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From: John Dickinson <jad@jadickinson.co.uk>
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Subject: Re: DNS-spoofing
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On 1 Aug 2008, at 01:54, Andrew Sullivan wrote:

> [no hat]
>
> On Thu, Jul 31, 2008 at 08:47:12PM +0200, Patrik Wallstrom wrote:
>> John Dickinson demonstrated on the dnsext wg meeting today that you  
>> can
>> spoof a local DNS reslover in 95ms. The resolver had a fixed source  
>> port.
>
> I understood from his remarks, also, that John hadn't seen anything
> except what had leaked.

That is correct. I read what was in a cache of the leaked blog post  
and I did see the metasploit code that was linked to on this list.  
However, this work is completely new code. I wrote it from scratch to  
make sure I fully understood the seriousness of the attack that was  
being suggested. Now I do! I hope this dispels any remaining myths  
about the need to deploy patches and DNSSEC.

As the people in the room will have seen, the time taken to succeed  
varies and 95ms was one of the better efforts. My suspicion is that  
there are a variety of ways to optimize this and I hope to do further  
work on that. However, I will not publish any details until after Aug  
6th.

Several people have asked if they can get the a copy of the code -  
While I am happy to do demos, I hope they will understand that this is  
not something that I want to release.

John

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From owner-namedroppers@ops.ietf.org  Fri Aug  1 05:50:27 2008
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Date: Fri, 1 Aug 2008 14:40:39 +0200
From: bert hubert <bert.hubert@netherlabs.nl>
To: namedroppers@ops.ietf.org
Subject: The math of kaminsky-spoofing a randomising source port resolver
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Hi everybody,

It was great fun to listen in on the DNSEXT meeting in Dublin yesterday. In
it I heard calls for understanding the problem better before rushing out
fixes, or even worse, a series of fixes that we ask people to install ASAP.

A few days ago I started to do the math on how hard it is to
'kaminksy-spoof' a fully randomised source port resolver. This message will
not elaborate on Dan's finding beyond the fact that it allows an attacker a
near infinite amount of chances to spoof a question.

The math is fairy trivial, but as I'm no expert it took me some time. I've
asked Evgeniy Polyakov and Jasper Spaans to read over my work, and they
found no obvious mistakes in it. But do take care, this stuff is fresh, and
I am a physics dropout!

The math
--------

I use the same symbols as in
http://tools.ietf.org/html/draft-ietf-dnsext-forgery-resilience#section-7.2
It may be instructive to read this section before delving into the rest of
this message.

      I: Number distinct IDs available (maximum 65536)

      P: Number of ports used (maximum around 64000 as ports under 1024
      are not always available, but often 1)

      N: Number of authoritative nameservers for a domain (averages
      around 2.5)

      F: Number of 'fake' packets sent by the attacker

      R: Number of packets sent per second by the attacker

      W: Window of opportunity, in seconds.  Bounded by the response
      time of the authoritative servers (often 0.1s)

      D: Average number of identical outstanding queries of a resolver
      (typically 1, see Section 5)

The combined chance to succeed with a single 'non-kaminsky spoofing
attempt':

   If the Window of opportunity length is 'W' and the attacker can send
   'R' packets per second, the number of fake packets 'F' that are
   candidates to be accepted is:

                          D * R * W
   F = R * W  ->   P_s  = ---------
                          N * P * I

Let's assume 'R' is fixed (it is a property of the network between the
attacker and the resolver).

Each spoofing attempt outlined above takes 'W' seconds. This means that if
you have T seconds for your attempt, you can perform T/W separate attacks.

The combined chance for success then becomes:

                       T/W
P_cs = 1 - ( 1 - P_s) 

If we put some common numbers in P_s, with source port randomization, we
find that P_s is really really small - P*I is in the order of 4*2^32,
whereas D, R and W are rather small (say 1, 100k and 0.1).

The approximation of P_cs is therefore:

WARNING: The approximation I use only applies for source port randomized
servers, otherwise the error is too big. It also does not hold for large
values of T!

             T * P_s             T * D * R
P_cs =      ---------      =     ---------
                W                N * P * I

Note how 'W' (the latency with the authentic auth server) fell out of the
equation!

Plugging in some common numbers, this gives:

P_cs = H * R / 1150000

Where H is the number of hours allotted. Again note that this is an
approximation,.

The full formula, which holds for larger values of R and T:

                               T / W                              10 * T
            (      D * R * W )                 (           R    )
P_cs  = 1 - ( 1 -  --------- )          =  1 - ( 1 -  --------- )         
            (      N * P * I )                 (        4.2e10  )


A caveat is that this math does not take into account the packet that asks
the original question, which happens once every 'W' seconds. The numbers on
the right also assume you can guess the authoritative nameserver that you
need to spoof.

If you plug in some realistic numbers in the P_cs formula, the chance of
succesfully spoofing a domain within two hours is around 8.1%, assuming you
can get 50000 packets/second to arrive at the resolver.

This will have cost you in the order of 1.5-2 gigabyte of packets though.

After 24 hours, the chance rises to around 64% - costing your 0.4TB of packets.

For your gnuplotting pleasure:
D=1.0
R=5000.0
W=0.1
N=1.0
P=64512
I=65535

Pcs(t) = 1 - (1 - ((D*R*W)/(N*P*I)))**(t/W)

Discussion
----------

If you delve into this deeper, it is also possible to do 'front loaded'
attacks where you do not wait out the full 'W' time window, but start on a
new question after (say) 0.1W already. This turns out not to disturb the
numbers measurably.

Evgeniy also did the math for not randomly blasting source port*ID packets,
but to make sure no duplicates are transmitted, and this turns out not to
matter a lot either.

The numbers above are all for 'perfect spoofing' - in actual life, packets
will get dropped, or the authentic authoritative server gets its answer in
quicker etc, so expect real life performance to be worse (or from our
perspective, 'better').

Interestingly, setting P=1 predicts very perfect chances of spoofing within 4-8
seconds - about in line with what the exploits out there achieve on
non-source port randomised servers.

The calculations above do not hold for nameservers that drop a query in case
of a detected spoofing attempt (when it sees too many "near misses"). This
technique does not invalidate the repeatability of the Kaminksy-technique,
but does minimise the chances of each individual spoof succeeding. There is
a reasonably popular resolver out there with such spoofing detection.

Smarter techniques?
-------------------
It may be possible that there are smarter, more adaptive ways to spoof a
server. But so far I haven't found them. Evgeniy is the kind of genius
however that I expect will discover new techniques if they exist - he is
currently working on his code.

Conclusion
----------
Even a perfectly source port randomized server can be spoofed, but it takes
real work and real amounts of time. More work is needed to protect the DNS.

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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From owner-namedroppers@ops.ietf.org  Fri Aug  1 06:33:25 2008
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Date: Fri, 01 Aug 2008 14:25:34 +0100
From: Alex Bligh <alex@alex.org.uk>
Reply-To: Alex Bligh <alex@alex.org.uk>
To: bert hubert <bert.hubert@netherlabs.nl>, namedroppers@ops.ietf.org
cc: Alex Bligh <alex@alex.org.uk>
Subject: Re: The math of kaminsky-spoofing a randomising source port
 resolver
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Bert,

--On 1 August 2008 14:40:39 +0200 bert hubert <bert.hubert@netherlabs.nl> 
wrote:

>              T * P_s             T * D * R
> P_cs =      ---------      =     ---------
>                 W                N * P * I

I see nothing wrong in your maths. Taking it from this stage
put in (as you suggest)
 D=1
 N=2.5
 I=65536
And look for P_cs=0.5

0.5 = T * 1 * R
      ----------
      2.5 * P * 65536

T = 81920 * P / R (seconds, for a 50% success rate)
Or
R = 81920 * P / T

So, for an attack on a non randomised port (P=1) to be more likely to
succeed than not within 100ms, you need approx 82,000 pps. Assuming Malory
is prepared to wait a day for his attack, he only needs to send one packet
every 10 seconds (practically undetectable).

With port randomisation (P=64000), Malory will need approximately 64,000
pps to have an even chance of a successful attack within a day.

Due to the effect of caching, Malory can presumably stop his attack when he
has a first successful hit, and the record will remain for just as long as
the TTL of the spoofed record.

This is assuming Malory doesn't do anything intelligent to speed up
his attack or parallelise multiple attacks, which would of course
make things easier.

It goes without saying that it would be trivial to orchestrate an attack
that focused solely on nameservers with low values of P, as (e.g.) the
OARC test demonstrate it's possible to guess this remotely.

Alex

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To: Thierry Moreau <thierry.moreau@connotech.com>
CC: Eric Rescorla <ekr@networkresonance.com>, namedroppers@ops.ietf.org
Subject: Re: transaction security in the last mile
References: <5721.1216397728@nsa.vix.com>	<87abgfosmc.fsf@mid.deneb.enyo.de>	<g5qved$ota$1@sf1.isc.org>	<g3tzem5tql.fsf@nsa.vix.com>	<48832197.80603@links.org>	<46510.1216569565@nsa.vix.com>	<20080720172348.CC45050846@romeo.rtfm.com>	<63353.1216579390@nsa.vix.com>	<20080720224723.A215850846@romeo.rtfm.com>	<48841429.6050905@links.org> <20080721044832.BA391498162@kilo.rtfm.com> <4884966D.2070801@connotech.com>
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Thierry Moreau wrote:
> 
> 
> Eric Rescorla wrote:
> 
>> At Mon, 21 Jul 2008 05:44:25 +0100,
>> Ben Laurie wrote:
>>
>>> Eric Rescorla wrote:
>>>
>>>>
>>>> So, I'm not saying that l-o-f will necessarily work here, but
>>>> I don't think it's necessary to prompt the user. Rather, you
>>>> can just accept the first key you see...
>>>
>>> And prompt them when it changes?
>>
>>
>> Good question. Probably retry via the original channel. I agree it's
>> not a real adequate answer...
>>
> 
> This is the pervasive question for almost all security schemes. How does 
> a client system establish, and then "maintain", trust in a remote party 
> which you (the designer, with your opinion perhaps reflected reflected 
> in a "policy") assume equiped with more skills in IT security management.
> 
> DNSEXT revisits this question because ... because what, I don't know. 
> Actually the question belongs to the IT security community of experts 
> which never addressed the question for what it is, i.e. pervasive for 
> almost all security schemes.

I think the security community has failed to grasp this nettle in many 
areas, not just the "trust" question (I dislike that word, but it is the 
term of art). In practice we've had the cryptographic and protocol 
answers to many security problems for a long time. What we have 
consistently failed to address is the fact that security is actually a 
UI problem, not a technical one.

Cheers,

Ben.

-- 
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From owner-namedroppers@ops.ietf.org  Sun Aug  3 07:05:01 2008
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From: Duane <duane@e164.org>
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Subject: Re: transaction security in the last mile
References: <5721.1216397728@nsa.vix.com>	<87abgfosmc.fsf@mid.deneb.enyo.de>	<g5qved$ota$1@sf1.isc.org>	<g3tzem5tql.fsf@nsa.vix.com>	<48832197.80603@links.org>	<46510.1216569565@nsa.vix.com>	<20080720172348.CC45050846@romeo.rtfm.com>	<63353.1216579390@nsa.vix.com>	<20080720224723.A215850846@romeo.rtfm.com>	<48841429.6050905@links.org> <20080721044832.BA391498162@kilo.rtfm.com> <4884966D.2070801@connotech.com> <48959C2C.4010107@links.org>
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Ben Laurie wrote:

> I think the security community has failed to grasp this nettle in many
> areas, not just the "trust" question (I dislike that word, but it is the

Try 'confidence' instead, as I keep saying every time it comes up, the
term 'trust' has been abused by cryptographers for a very long time, and
the term only makes sense after a continued relationship to determine if
you trust the other party or not. After all would you 'trust' someone
with your car or your child just because they have a SSL certificate
that is signed by a company with their root certificate in the browser?

Where as the term 'confidence' you place a level of confidence in seeing
the lock that the connection is encrypted, you have a level of
confidence that most companies, most of the time

> term of art). In practice we've had the cryptographic and protocol
> answers to many security problems for a long time. What we have
> consistently failed to address is the fact that security is actually a
> UI problem, not a technical one.

I think things are actually going backwards to be honest, the way
firefox (it's the worst offender now) and other browsers treat invalid
and self signed certs means most if not all people that could benefit
from at least self signed certs don't use any encryption to prevent
pop-up messages from pestering everyone to death.

It really is to the detriment of everyone that some of these snake oil
sales men have pushed things in this direction.

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Sun Aug  3 11:17:16 2008
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From: bert hubert <bert.hubert@netherlabs.nl>
To: namedroppers@ops.ietf.org
Subject: Some lighter thoughts..
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In jest, but I was reading 'The trouble with physics'
http://www.thetroublewithphysics.com/ and the resemblance struck me :-)

For more about this 11 or 26-dimensional theory, head to
http://en.wikipedia.org/wiki/String_Theory

The Top-10 Reasons Why DNSSEC Is the String Theory of the Internet
------------------------------------------------------------------
10. Adds many new dimensions to an already complex problem
 9. Hogs all the research funds
 8. Has many careers riding on it
 7. Widely hailed by expert and layman alike as the next big thing
 6. Responds to shortcomings by reinventing itself and doubling its
    complexity
 5. On its third iteration to succes
 4. Attracts the brightest minds of the industry
 3. Cult-like following among believers
 2. Always on the verge of solving a real world problem
 1. Will be ready in 6 months!


-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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From owner-namedroppers@ops.ietf.org  Mon Aug  4 03:52:49 2008
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Date: Mon, 4 Aug 2008 12:45:02 +0200
From: bert hubert <bert.hubert@netherlabs.nl>
To: namedroppers@ops.ietf.org
Subject: correction! Re: The math of kaminsky-spoofing a randomising source port resolver
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On Fri, Aug 01, 2008 at 02:40:39PM +0200, bert hubert wrote:
> If you plug in some realistic numbers in the P_cs formula, the chance of
> succesfully spoofing a domain within two hours is around 8.1%, assuming you
> can get 50000 packets/second to arrive at the resolver.
> 
> This will have cost you in the order of 1.5-2 gigabyte of packets though.
> 
> After 24 hours, the chance rises to around 64% - costing your 0.4TB of packets.

The first gigabyte number is wrong - 2 hours of this will cost you around
36GB of packets. 24 hours around 0.4TB of packets.

This is assuming 100 bytes per attempt, which at 50000 packets/s is around
40 megabits/s. Given some overhead, make it a good 50 megabits/s.

        Bert

-- 
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To: bert hubert <bert.hubert@netherlabs.nl>
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Subject: Re: correction! Re: The math of RFC3822.2.2-spoofing a randomising
 source port resolver
References: <20080801124038.GA5994@outpost.ds9a.nl> <20080804104502.GA32568@outpost.ds9a.nl>
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bert hubert wrote:

> correction! Re: The math of kaminsky-spoofing a randomising source port resolver

Why do you call such a well known vulnerability of DNS, which was
documented in section 2.2 of RFC3822 in 2004 several years after it
had been publicly known, kaminsky-spoofing?

> This is assuming 100 bytes per attempt, which at 50000 packets/s is around
> 40 megabits/s. Given some overhead, make it a good 50 megabits/s.

Your bandwidth figure is applicable to attackers but not to victims of
the attackers attacking many victims at once.

So, if an attacker have 1000 victims, the attacker needs 1/1000 less
time to compromise one or more victims of the attacker than an attacker
with only one victim and each victim feel 1/1000 less amount of traffic.

							Masataka Ohta


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From owner-namedroppers@ops.ietf.org  Mon Aug  4 07:05:10 2008
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Subject: Re: correction! Re: The math of RFC3822.2.2-spoofing a randomising source port resolver
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* Masataka Ohta:

> bert hubert wrote:
>
>> correction! Re: The math of kaminsky-spoofing a randomising source port =
resolver
>
> Why do you call such a well known vulnerability of DNS, which was
> documented in section 2.2 of RFC3822 in 2004 several years after it
> had been publicly known, kaminsky-spoofing?

I think you mean section 2.3 of RFC 3822.  I agree that the basic
attack is presented in that section.

I'm not sure if the authors were fully aware of the implications.  I
guess ISC would have rolled out source port randomization a long time
ago if they were.

> So, if an attacker have 1000 victims, the attacker needs 1/1000 less
> time to compromise one or more victims of the attacker than an attacker
> with only one victim and each victim feel 1/1000 less amount of traffic.

Correct.  And as we've seen over and over again, you can actually
monetize attacks even if you don't know the identities of your victims
before you start the attack, so it's a real problem.

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=DFe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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To: namedroppers@ops.ietf.org
Subject: Re: correction! Re: The math of RFC3822.2.2-spoofing a randomising source port resolver 
In-reply-to: Your message of Mon, 04 Aug 2008 15:57:17 +0200.
             <82hca0khmq.fsf@mid.bfk.de> 
Date: Mon, 04 Aug 2008 16:18:21 +0200
From: Jaap Akkerhuis <jaap@NLnetLabs.nl>
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    >
    > Why do you call such a well known vulnerability of DNS, which was
    > documented in section 2.2 of RFC3822 in 2004 several years after it
    > had been publicly known, kaminsky-spoofing?
    
    I think you mean section 2.3 of RFC 3822.  I agree that the basic
    attack is presented in that section.
    
There is no section 2.3 in RFC 3822. That RFC is about "Finding
Fibre Channel over TCP/IP (FCIP) Entities Using Service Location
Protocol version 2 (SLPv2)" so I'm a bit lost where you all are
talking about.

	jaap


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From: Paul Vixie <vixie@isc.org>
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In-Reply-To: Your message of "Mon, 04 Aug 2008 15:57:17 +0200."
             <82hca0khmq.fsf@mid.bfk.de> 
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> From: Florian Weimer <fweimer@bfk.de>
> 
> * Masataka Ohta:
> > Why do you call such a well known vulnerability of DNS, which was
> > documented in section 2.2 of RFC3822 in 2004 several years after it
> > had been publicly known, kaminsky-spoofing?
> 
> I think you mean section 2.3 of RFC 3822.  I agree that the basic
> attack is presented in that section.
> 
> I'm not sure if the authors were fully aware of the implications.  I
> guess ISC would have rolled out source port randomization a long time
> ago if they were.

indeed, noone on earth knew that this could be done in 11 seconds until
february 2008.  given the severe trauma caused by udp port randomization
for firewalls and NATs and solaris-10 and so on, i think there was a real
and correct cost-benefit tradeoff being made when this attack took days
or weeks of sustained multimegabit traffic to pull off.

> > So, if an attacker have 1000 victims, the attacker needs 1/1000 less
> > time to compromise one or more victims of the attacker than an attacker
> > with only one victim and each victim feel 1/1000 less amount of traffic.
> 
> Correct.  And as we've seen over and over again, you can actually
> monetize attacks even if you don't know the identities of your victims
> before you start the attack, so it's a real problem.

agreed.  my two even-worse-case scenarios for this have been every bot
doing a short 200-packet attack on some random RDNS every time it's about
to go back into its wait-for-command mode, and then the high-fanout mode
described above by masataka.  if the attacker's goal is to drive traffic
to a phishing site, then rather than think of creative ways to spell ebay's
or paypal's or a bank's URI-domain, or hiding that spelling behind images
or javascript, they can just toss their seeds into the wind and let them
sprout where they may.  (i live outside any city, and i have great respect
for the power of weeds and wild grasses to gradually take over every open
acre.)

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Subject: Re: correction! Re: The math of RFC3822.2.2-spoofing a randomising source port resolver
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From: Florian Weimer <fweimer@bfk.de>
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* Jaap Akkerhuis:

>     >
>     > Why do you call such a well known vulnerability of DNS, which was
>     > documented in section 2.2 of RFC3822 in 2004 several years after it
>     > had been publicly known, kaminsky-spoofing?
>=20=20=20=20=20
>     I think you mean section 2.3 of RFC 3822.  I agree that the basic
>     attack is presented in that section.
>=20=20=20=20=20
> There is no section 2.3 in RFC 3822.

RFC 3833, sorry.  *argh*

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=DFe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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From: Stefan Schmidt <zaphodb@zaphods.net>
To: namedroppers@ops.ietf.org
Subject: Re: correction! Re: The math of RFC3822.2.2-spoofing a randomising
	source port resolver
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On Mon, Aug 04, 2008 at 02:22:41PM +0000, Paul Vixie wrote:
> > I'm not sure if the authors were fully aware of the implications.  I
> > guess ISC would have rolled out source port randomization a long time
> > ago if they were.
> 
> indeed, noone on earth knew that this could be done in 11 seconds until
> february 2008.  given the severe trauma caused by udp port randomization
> for firewalls and NATs and solaris-10 and so on, i think there was a real
> and correct cost-benefit tradeoff being made when this attack took days
> or weeks of sustained multimegabit traffic to pull off.

Tradeoff yes, trauma not really for that is something that requires a shock.
You knew that this patch needed some ironing out and that the best way of
achieving that is to just roll it out, no need to be shocked about that now.

When i switched our recursive DNS from BIND9 to PowerDNS recursor in 2006 i
was surprised that the recursor didn't use up more system resources than BIND9
even so it did randomize the query port. Apparently this can be done right
and from what i hear this also works pretty well on Solaris installations.

For years before my switch i wondered why ISC did not simply use Linux' epoll
or FreeBSD's kqueue where available, how about you?

	Stefan
-- 
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> From: Stefan Schmidt <zaphodb@zaphods.net>
> 
> On Mon, Aug 04, 2008 at 02:22:41PM +0000, Paul Vixie wrote:
> > indeed, noone on earth knew that this could be done in 11 seconds until
> > february 2008.  given the severe trauma caused by udp port randomization
> > for firewalls and NATs and solaris-10 and so on, i think there was a real
> > and correct cost-benefit tradeoff being made when this attack took days
> > or weeks of sustained multimegabit traffic to pull off.
> 
> Tradeoff yes, trauma not really for that is something that requires a shock.
> You knew that this patch needed some ironing out and that the best way of
> achieving that is to just roll it out, no need to be shocked about that now.

let's be clear about this.  neither dnscache nor powerdns was creating as many
simultaneous upstream flows in those years as the kaminsky defense requires,
and the market size for these tools was in those years so small that many of
the firewall / NAT / kernel instabilities BIND is running into as we deploy 
UDP port randomization were simply not encountered until now.

smaller and less popular implementations need have no fear of damaging their
reputations by being seen "legislating from the bench".  in BIND's case we are
not able to adopt simplistic attitudes like "requires a shock" lest our user
community storm our front yard with torches and pitchforks in hand.

that's why the nuanced view of this is as a "real and correct cost-benefit
tradeoff".  now that kaminsky changed the costs and benefits, ISC has adapted.

> When i switched our recursive DNS from BIND9 to PowerDNS recursor in 2006
> i was surprised that the recursor didn't use up more system resources
> than BIND9 even so it did randomize the query port. Apparently this can
> be done right and from what i hear this also works pretty well on Solaris
> installations.

see above.

> For years before my switch i wondered why ISC did not simply use Linux'
> epoll or FreeBSD's kqueue where available, how about you?

because it didn't make any performance difference for the number of
descriptors we had open simultaneously, this was another cost-benefit
tradeoff.  there was insufficient need to justify the complexity.  post
kaminsky, there is sufficient need to justify the complexity.

> "cron loves you too, that's why it sends you so much mail."
> - Paul Vixie, author of Vixie Cron

:-).

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From owner-namedroppers@ops.ietf.org  Mon Aug  4 10:53:09 2008
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To: namedroppers@ops.ietf.org
Subject: Large EDNS0 buffer sizes and IPv6
From: Florian Weimer <fweimer@bfk.de>
Date: Mon, 04 Aug 2008 19:45:18 +0200
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How do you make large EDNS0 buffer sizes work with IPv6?  I couldn't
find anything about that in the RFC or in the draft.

Unlike IPv4, IPv6 doesn't fragment in the core.  This means that the
source must perform path MTU discovery and fragment on its own.  This,
in turn, requires client-specific state, which is generally considered
a bad thing.

What am I missing?

Apparently, this was raised by Itojun at IETF48 back in 2000, but I
don't see how it was resolved.  Implementations with buffer sizes
greater than 1400 bytes seem to fragment according to the link MTU
they are connected to, and do not care about the path MTU.  (I haven't
got native IPv6, so it's hard for me to tell what's going on.)

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=DFe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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From owner-namedroppers@ops.ietf.org  Mon Aug  4 12:29:03 2008
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From: Bryan Seitz <seitz@bsd-unix.net>
To: namedroppers@ops.ietf.org
Subject: Re: correction! Re: The math of RFC3822.2.2-spoofing a randomising
	source port resolver
Message-ID: <20080804192337.GA88503@bsd-unix.net>
References: <20080801124038.GA5994@outpost.ds9a.nl> <20080804104502.GA32568@outpost.ds9a.nl> <4896FA14.2030103@necom830.hpcl.titech.ac.jp> <82hca0khmq.fsf@mid.bfk.de> <18763.1217859761@nsa.vix.com> <20080804155217.GL18233@zaphods.net> <34451.1217868477@nsa.vix.com>
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On Mon, Aug 04, 2008 at 04:47:57PM +0000, Paul Vixie wrote:
> > From: Stefan Schmidt <zaphodb@zaphods.net>
> > 
> > On Mon, Aug 04, 2008 at 02:22:41PM +0000, Paul Vixie wrote:
> > > indeed, noone on earth knew that this could be done in 11 seconds until
> > > february 2008.  given the severe trauma caused by udp port randomization
> > > for firewalls and NATs and solaris-10 and so on, i think there was a real
> > > and correct cost-benefit tradeoff being made when this attack took days
> > > or weeks of sustained multimegabit traffic to pull off.
> > 
> > Tradeoff yes, trauma not really for that is something that requires a shock.
> > You knew that this patch needed some ironing out and that the best way of
> > achieving that is to just roll it out, no need to be shocked about that now.
> 
> let's be clear about this.  neither dnscache nor powerdns was creating as many
> simultaneous upstream flows in those years as the kaminsky defense requires,
> and the market size for these tools was in those years so small that many of
> the firewall / NAT / kernel instabilities BIND is running into as we deploy 
> UDP port randomization were simply not encountered until now.
> 

FYI,

   In early 2006 I migrated approximately 120 BIND nameserver installations down to
approximately 30 PowerDNS installations for a very large ISP.  This migration not only 
allowed us to scale down the number of servers and save money on server hardware, but 
also improved query latencies and increased security due to port randomization. Thus,
source port randomization did not have an impact performance and we were able to reduce 
our server count by a factor of 4.

> > "cron loves you too, that's why it sends you so much mail."
> > - Paul Vixie, author of Vixie Cron
> 
> :-).

it sure does ;)

-- 
             
Bryan G. Seitz

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From owner-namedroppers@ops.ietf.org  Mon Aug  4 13:13:39 2008
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Date: Mon, 4 Aug 2008 16:06:26 -0400
From: Andrew Sullivan <ajs@commandprompt.com>
To: namedroppers@ops.ietf.org
Subject: NomCom call for volunteers
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Dear colleagues,

At the request of the Nomcom Chair, I'm sending this reminder that he
is looking for volunteers to serve.  For more information on this,
including eligibility criteria and selection procedures, please have a
look at the message the Nomcom Chair sent:

https://datatracker.ietf.org/ann/nomcom/1617/

Best regards,

Andrew

-- 
Andrew Sullivan
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http://www.commandprompt.com/

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From owner-namedroppers@ops.ietf.org  Mon Aug  4 14:04:31 2008
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Subject: Re: correction! Re: The math of RFC3822.2.2-spoofing a randomising source port resolver
Date: Mon, 4 Aug 2008 22:56:36 +0200
References: <20080801124038.GA5994@outpost.ds9a.nl> <20080804104502.GA32568@outpost.ds9a.nl> <4896FA14.2030103@necom830.hpcl.titech.ac.jp> <82hca0khmq.fsf@mid.bfk.de> <18763.1217859761@nsa.vix.com>  <20080804155217.GL18233@zaphods.net>  <34451.1217868477@nsa.vix.com>
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On 04.08.2008, at 18:47, Paul Vixie wrote:

> let's be clear about this.  neither dnscache nor powerdns was  
> creating as many
> simultaneous upstream flows in those years as the kaminsky defense  
> requires,

There you lost me, i am totally unclear what you mean by upstream flows.
In case of PowerDNS recursor:
Less outgoing queries per recursive lookup, true, but that did not  
change post 'kaminsky'.
As for releases i don't consider OS distributions upstream but anyway  
there had been some.

> and the market size for these tools was in those years so small that  
> many of
> the firewall / NAT / kernel instabilities BIND is running into as we  
> deploy
> UDP port randomization were simply not encountered until now.

True if you're counting market size in deployments and not users served.

> smaller and less popular implementations need have no fear of  
> damaging their
> reputations by being seen "legislating from the bench".  in BIND's  
> case we are
> not able to adopt simplistic attitudes like "requires a shock" lest  
> our user
> community storm our front yard with torches and pitchforks in hand.
>
> that's why the nuanced view of this is as a "real and correct cost- 
> benefit
> tradeoff".  now that kaminsky changed the costs and benefits, ISC  
> has adapted.

So smaller is easier and closer to the community.
Sounds like better to me. *scnr*

   Stefan
--
"Since light travels faster than sound, people appear bright until you  
hear
them speak."
- anonymous


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From owner-namedroppers@ops.ietf.org  Mon Aug  4 14:08:21 2008
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Date: Mon, 4 Aug 2008 23:03:14 +0200
From: bert hubert <bert.hubert@netherlabs.nl>
To: namedroppers@ops.ietf.org
Subject: calculating the chance of spoofing an agile source port randomised resolver
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Dear working group,

This message sets out to calculate how hard it is to spoof a resolver that
takes simple, unilateral, steps to prevent such spoofing.

Unilateral in this case means that any resolver can implement these steps,
without changing the DNS protocol or authoritative server behaviour.
Everybody that implements the ideas below immediately improves the general
security of the DNS.

To save you all the reading, the simple unilateral measures can bring down
the chance to be spoofed to under 1% after a year of non-stop 50 megabit/s
packet blasting.

Note however that my math or my ideas may be wrong. Please read carefully!

Work so far
-----------
Recapping, calculations so far show that a fully source port randomized
nameserver can be spoofed with a 64% chance of success within 24 hours,
requiring around 0.4TB of packets to be generated. If 2 hours are available,
the chance of success is 8.1%.

This assumes that the attacker is able to generate around 50 megabits/s, and
also important, that the resolver is able to process 50k incoming responses/s.

Details are on
http://www.ops.ietf.org/lists/namedroppers/namedroppers.2008/msg01194.html
with the caveat that where it says "1.5 - 2 GB", it should say "36GB". 

Since that posting, quite a number of people have studied the calculations,
and they appear to hold up.

Note that the present post does not address the dangers created by those
able to actively intercept and modify traffic - people with such abilities
have little need to spoof DNS anyhow.

Situation
---------
The current situation is not acceptable - the resources needed to perform a
successful spoofing attack are available, if not generally, then to an
relevant subset of Internet users.

It turns out that it takes a lot of effort to get the world to apply even a
minor patch that has received tremendous front-page coverage on all the
security websites - the source port randomisation patches in this case.

So if we want to move quickly, we need a solution that can be rolled out
without having to upgrade large parts of the Internet.

Agile countermeasures
---------------------
There are a number of strategies a resolver could employ to make itself
effectively unspoofeable, some of these include:

A) Sending out questions over TCP/IP
B) Repeating questions a number of times, and requiring the answers to be
   equivalent

The problems with these two techniques is that they imply a certain overhead
and increase the general CPU utilization on the Internet.

Furthermore there are strategies that make spoofing harder, but not
impracticable:

C) Case games ('dns-0x20')
D) Use multiple source addresses
  
A very comprehensive enumeration of techniques can be found on
http://www.ops.ietf.org/lists/namedroppers/namedroppers.2008/msg01131.html

Sadly, it appears that on this impressive list there is nothing without more
or less unacceptable overhead that really gets us out of the woods, where
this is arbitrarily defined as reducing the spoofing success rate to below
1% after a year of non-stop trying at 50 megabit/s.

Detecting a spoofing attempt in progress
----------------------------------------
Since any spoofed response has a chance of around 2^-32 of being accepted,
it stands to reason around 2^31 bogus responses will arrive at the resolver
before the attacker manages to achieve his goals.

Since we know we have effective countermeasures available, like A and B
mentioned above, we could deploy these in case a spoofing attempt is
detected. Remember that A and B are generally available, but that we don't
want to resort to them all the time, for all domains, because of their
overhead.

Occasionally, port numbers get modified in transit. Additionally, responses
to queries sometimes arrive late enough that a new equivalent query has
since been sent. This means we should not consider a single response
mismatch to be a sign of a spoofing attempt in progress.

If we allow X mismatches before falling back on A or B, the chance of a
single query being spoofed is:

            X
        ---------  ~= 2^-32 * X
	N * P * I 

Assuming each individual attack lasts W seconds (being latency between the
authentic authoritative server and the resolver), the combined spoofing
chance after T seconds becomes:

                    T/W
1 - (1 - 2^-32 * X)       ~= 2^-32 * X * T/W

Putting in 20 for X and 0.1s for W, this gets us a combined spoofing chance
of 0.4% for a full day. Interesting, but not good enough, especially since
the attacker might well send only X packets per attempt, and launch far more
attempts.

However, if the attacker has a defined goal about what to spoof, each
successive attempt might be for a different domain name, or differ in other
respects, but all those attempts will share some characteristics.

Two things that will be identical, or at least reasonably unique are the
source address of the spoofed packet (aka, the network address of the
authentic authoritative server), plus the 'zone cut apex'. This last bit
requires some understanding of the way a resolver works.

(I made up this phrase, 'zone cut apex', but I think there are people with
better knowledge of DNS verbiage than I, I'd love to hear of a better name)

When a resolver asks NS1.EXAMPLE.COM for 'this.is.a.long.example.com', the
resolver knows it is asking NS1.EXAMPLE.COM in its role as 'EXAMPLE.COM'
nameserver - this is how it selected that server.

This means that an attacker might try many variations on
'this.is.a.long.example.com', what will remain identical is the 'zone cut
apex', which is 'EXAMPLE.COM'. What will also remain identical is the
(small) set of example.com servers available.

I'll get into more detail after Dan Kaminksy has held his presentation. The
upshot however is that multiple different attempts can be correlated, and
thus be counted together in the spoofing-detection counts.

If we conservatively decide to impose a 5 minute 'fallback to A or B'-regime
for a {source IP, zone cut apex}-tuple, and leave the detection limit at 20,
this means an attacker will have one chance every 5 minutes of getting in an
attempt.

This is equivalent to setting W equal to 300 seconds above, yielding us a
combined chance of spoofing a domain after a year of trying of 0.05%.

Well within our goal.

Reality intrudes
----------------
Sadly, the reality is that we won't recognize all spoofed packets that
guessed wrong, so to speak. Typical operating systems will only let a
nameserver know about packets that arrived on a socket open for that
purpose.

In the very worst case, the server is only listening on a single port, and
by the time a single mismatch is received by the nameserver process, on
average 32000 will have arrived on the network interface.

This means that in the calculation above, if we don't take additional
measures, we need to set X to 32000, leading to a combined *monthly*
spoofing chance of 6.4% (and a yearly near-certainty).

Fine tuning things
------------------
By raising the fallback period to an hour, the yearly spoofing chance
becomes 6.5%, assuming we only see 1 in every 32000 spoof attempts.

If in addition a small number of sockets is kept open, say 10, to function as
'canary ports', X reduces to 3200, and the yearly spoofing chance is back at
a low 0.65%.

Canary ports serve no function except to detect spoofing attempts. For
efficiency reasons, these ports may simply be ports that had previously been
used for source port randomisation, but kept around somewhat longer.

The number of canary ports, and the fallback period can be tuned at will to
achieve desired spoofing resilience levels.

Remaining Problems
------------------
Countermeasure 'A' does not work for domains not offering TCP service.
Countermeasure 'B' does not work for domains where single authoritative
servers generate differing answers to repetitive questions. This might
happen in case of (hardware) load balancers, or load balanced desynchronised
nameservers.

Best results might be achieved by alternately trying countermeasure A and B
- any server that does not support TCP *and* sends out inconsistent replies
is in for some tough love if someone attempts to spoof the domains it hosts.

Conclusion
----------
If the calculations and ideas elaborated above hold up, it appears feasible
to achieve arbitrarily low spoofing chances, without doing any further
protocol work.

Importantly, such changes would allow individual resolvers to protect their
users without having to wait for changes to all authoritative servers.

In other words, everybody who participates receives an immediate benefit.

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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From:	 JINMEI Tatuya / =?ISO-2022-JP?B?GyRCP0BMQEMjOkgbKEI=?=
 <Jinmei_Tatuya@isc.org>
To:	 Florian Weimer <fweimer@bfk.de>
Cc: 	 namedroppers@ops.ietf.org
Subject: Re: Large EDNS0 buffer sizes and IPv6
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At Mon, 04 Aug 2008 15:07:48 -0700,
JINMEI Tatuya <Jinmei_Tatuya@isc.org> wrote:

> > Apparently, this was raised by Itojun at IETF48 back in 2000, but I
> > don't see how it was resolved.  Implementations with buffer sizes
> > greater than 1400 bytes seem to fragment according to the link MTU
> > they are connected to, and do not care about the path MTU.  (I haven't
> > got native IPv6, so it's hard for me to tell what's going on.)
> 
> My understanding is that the name server is expected to set the
> IPV6_USE_MIN_MTU socket option (when available) for its AF_INET6 UDP
> sockets.  See RFC3542 for this option.  BIND9 does that; unbound also
> seems to do so according to a quick naive grep.

In this context I should have rather focused on authoritative
servers...for that matter, NSD also seems to do so according to a
quick naive grep.

---
JINMEI, Tatuya
Internet Systems Consortium, Inc.

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 <Jinmei_Tatuya@isc.org>
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Subject: Re: Large EDNS0 buffer sizes and IPv6
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At Mon, 04 Aug 2008 19:45:18 +0200,
Florian Weimer <fweimer@bfk.de> wrote:

> How do you make large EDNS0 buffer sizes work with IPv6?  I couldn't
> find anything about that in the RFC or in the draft.
> 
> Unlike IPv4, IPv6 doesn't fragment in the core.  This means that the
> source must perform path MTU discovery and fragment on its own.  This,
> in turn, requires client-specific state, which is generally considered
> a bad thing.
> 
> What am I missing?
> 
> Apparently, this was raised by Itojun at IETF48 back in 2000, but I
> don't see how it was resolved.  Implementations with buffer sizes
> greater than 1400 bytes seem to fragment according to the link MTU
> they are connected to, and do not care about the path MTU.  (I haven't
> got native IPv6, so it's hard for me to tell what's going on.)

My understanding is that the name server is expected to set the
IPV6_USE_MIN_MTU socket option (when available) for its AF_INET6 UDP
sockets.  See RFC3542 for this option.  BIND9 does that; unbound also
seems to do so according to a quick naive grep.

---
JINMEI, Tatuya
Internet Systems Consortium, Inc.

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On 04.08.2008, at 18:47, Paul Vixie wrote:

> let's be clear about this.  neither dnscache nor powerdns was  
> creating as many
> simultaneous upstream flows in those years as the kaminsky defense  
> requires,

Thanks to another reader of this list the penny dropped. ;)
By 'kaminsky defense' you probably referred to the 'repeat the query n- 
times' or 'fallback to tcp' methods that were under discussion mostly  
on dns-operations@ and i thought you were referring to the mere port  
randomization.

What Bert Hubert's math is saying is that it requires a tremendous  
amount of time and packets to successfully spoof a recursive  
nameserver that uses good randomness on both query id and source port  
selection.
I won't say we're safe now, but i think he has proven that - if done  
right - it buys us enough time so that we do not need to rush into  
approving the next best thing.

As to catch up with another subthread: The 'Kaminsky Exploit/Bug/ 
Problem' is in the press and Dan is getting most of the credit for it,  
thats done, no way around it. I think calling it the Kaminsky whatever  
for now just simplifies referencing and makes it easier for people to  
follow the discussion. Lets just make sure we don't create a 'Kaminsky- 
RFC'.

  Stefan

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> There you lost me, i am totally unclear what you mean by upstream flows.

ok, never mind.

> > and the market size for these tools was in those years so small that ...
> 
> True if you're counting market size in deployments and not users served.

i was not distinguishing.  we could argue about that distinction in today's
world but i was referring to "in those years" which was yesterday's world
and there is no argument to be made about that distinction historically.

> > smaller and less popular implementations need have no fear of damaging
> > their reputations by being seen "legislating from the bench".  in
> > BIND's case we are not able to adopt simplistic attitudes like
> > "requires a shock" lest our user community storm our front yard with
> > torches and pitchforks in hand.
> >
> > that's why the nuanced view of this is as a "real and correct cost-
> > benefit tradeoff".  now that kaminsky changed the costs and benefits,
> > ISC has adapted.
> 
> So smaller is easier and closer to the community.
> Sounds like better to me. *scnr*

smaller may be easier, but open source is either close to the community or
it's dead, so smaller isn't any closer to the community.  ISC chooses to
serve the largest possible community, and so we avoid ramming things down
the community's throat -- no "shocks" come through us.  amusingly, some of
the later-coming f/l/oss dns implementors have claimed that ISC was failing
to serve the community because we didn't shock enough, and others said we
were failing to serve the community because we shocked too often, and some
have even said that we got it wrong both ways.

followups to dnsops, please -- this thread isn't about the protocol any more.

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-----BEGIN PGP SIGNED MESSAGE-----
Hash: SHA1

Hi Bert,

You seem to be hard at work continuing the forgery resilience
calculations for this new vulnerability.  I would suggest this is not
something for the forgery-resilience draft that is in WGLC right now?

The calculations are interesting, but I would prefer to discuss after
the full disclosure.  This means that informed opinions can be given
instead of vague guesses.

I think your baseline is wrong.  You quote 24 hours for one unpatched
chance?  But in the dnsext working group we saw 95 msec easily achieved?
There must be something wrong here.  This would bring the one year final
result here down to 0.095 / (24*3600) of a year time (about 30 seconds).

| Since that posting, quite a number of people have studied the
calculations,
| and they appear to hold up.

Where was that?

| Note that the present post does not address the dangers created by those
| able to actively intercept and modify traffic - people with such abilities
| have little need to spoof DNS anyhow.

Well they do, but not criminally so. (it may be an unethical action)

| Agile countermeasures
| The problems with these two techniques is that they imply a certain
overhead
| and increase the general CPU utilization on the Internet.

Yes, we lack good countermeasures.

Except for DNSSEC.  DNSSEC is a very good countermeasure.  Good protocol
work.  Serious data protection.  The protocol and software
implementations have just been completed end of last year (when DNSEXT
went to sleep).  But it seems that it needs some time before everyone
can deploy this.  I read your post as looking for interim solutions, to
buy the internet time to deploy DNSSEC.

| Detecting a spoofing attempt in progress
| the attacker might well send only X packets per attempt, and launch
far more
| attempts.

See Masataka Ohta's post.  Detection may not work well at all, and as
you argue can easily be circumvented.

| (I made up this phrase, 'zone cut apex', but I think there are people with
| better knowledge of DNS verbiage than I, I'd love to hear of a better
name)
| I'll get into more detail after Dan Kaminksy has held his
presentation. The
| upshot however is that multiple different attempts can be correlated, and
| thus be counted together in the spoofing-detection counts.

Zone cut apex idea.  Well I think I understand what you mean with zone
cut apex, at least :-)

| Conclusion
| ----------
| If the calculations and ideas elaborated above hold up, it appears
feasible
| to achieve arbitrarily low spoofing chances, without doing any further
| protocol work.

Unfortunately, I do not think the above holds up.

| Importantly, such changes would allow individual resolvers to protect
their
| users without having to wait for changes to all authoritative servers.
|
| In other words, everybody who participates receives an immediate benefit.

This is certainly a good property for solutions (i.e. like 0x20 has).

Best regards,
~   Wouter
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From owner-namedroppers@ops.ietf.org  Tue Aug  5 01:22:01 2008
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From: bert hubert <bert.hubert@netherlabs.nl>
To: Wouter Wijngaards <wouter@NLnetLabs.nl>
Cc: namedroppers@ops.ietf.org
Subject: Re: calculating the chance of spoofing an agile source port randomised  resolver
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On Tue, Aug 05, 2008 at 09:32:33AM +0200, Wouter Wijngaards wrote:
> You seem to be hard at work continuing the forgery resilience
> calculations for this new vulnerability.  I would suggest this is not
> something for the forgery-resilience draft that is in WGLC right now?

This is most definitely not for the draft, which I consider wrapped up and
finished. 

> I think your baseline is wrong.  You quote 24 hours for one unpatched
> chance?  But in the dnsext working group we saw 95 msec easily achieved?

I quote 4-8 seconds for very high chances of success, which is very much in
line with what was demonstrated at the working group:

  Interestingly, setting P=1 predicts very perfect chances of spoofing within
  4-8 seconds - about in line with what the exploits out there achieve on
  non-source port randomised servers.

>From the working group demo, I recall the attack succeeding most of the
time, and taking a number of seconds on average. 

> | Since that posting, quite a number of people have studied the calculations,
> | and they appear to hold up.
> 
> Where was that?

On namedroppers and dns-operations. Alex Bligh and Florian Weimer commented
specifically on the lists, Evgeniy Polyakov and Jasper Spaans also verified
the calculations, off-list. 

> went to sleep).  But it seems that it needs some time before everyone
> can deploy this.  I read your post as looking for interim solutions, to
> buy the internet time to deploy DNSSEC.

Well - I personally would not bet on DNSSEC ever being deployed fully. But
that is irrelevant to the discussion - my post is indeed about what can and
perhaps needs to be done today, by any resolver on the internet.

> | Detecting a spoofing attempt in progress
> | the attacker might well send only X packets per attempt, and launch
> far more
> | attempts.
> 
> See Masataka Ohta's post.  Detection may not work well at all, and as
> you argue can easily be circumvented.

Hmm - I may be wrong, but I've given it a lot of thought and I don't see how
the detection can easily be circumvented. Any individual spoofing attack is
overwhelmingly likely to fail, and can hence be detected safely.

But it would be very good to see if we as a working group could punch
practical holes in this. Our track record is not perfect, we did not see
everything coming, but the brightest minds of DNS do hang out here.

Regarding what Masataka Ohta says, I don't fully understand what he means,
but I think what he says does not mean spoofing detection can be evaded
easily.

	Bert

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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From owner-namedroppers@ops.ietf.org  Tue Aug  5 01:33:30 2008
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Date: Tue, 05 Aug 2008 09:25:49 +0100
From: Alex Bligh <alex@alex.org.uk>
Reply-To: Alex Bligh <alex@alex.org.uk>
To: Wouter Wijngaards <wouter@NLnetLabs.nl>,
 bert hubert <bert.hubert@netherlabs.nl>
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 randomised resolver
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--On 5 August 2008 09:32:33 +0200 Wouter Wijngaards <wouter@NLnetLabs.nl> 
wrote:

>| Since that posting, quite a number of people have studied the
> calculations,
>| and they appear to hold up.
>
> Where was that?

I verified Bert's formulae down to the point I snipped in my email. I did
not verify the numbers he plugged in (I couldn't quite see where he
was going) but I did calculate using his formulae the packet rate
required where an attack on an unpatched server was more likely than
not to yield in less than 100ms (the "John Dickinson number"). This
was 82,000 pps (manageable, just, but then John said he demonstrated
it yielded once in less than 100ms - to have a 1 in 20 chance of succeeding
you'd only need 8,200 pps).

The read I took from Bert's calculations (which I think is different
from the read Bert took) was:
* Brute forcing the calculations shows that there is still a risk with
  port randomisation
* The situation is even worse if NAT is involved
* There are several possible bits of cleverness one could add that would
  make attacks (a) more effective and (b) less detectable. I left a large
  hint as to one of these but don't really want to spell it out on a
  public mailing list.

These leads me to believe that port randomisation is insufficient as
a solution. I believe the extra tweaks (canary ports etc.) are just
as likely to lead to DoS vectors as improved security.

I realise this may not be quite where Bert was driving, but I do
agree with the formula part of his maths.

>| The problems with these two techniques is that they imply a certain
> overhead
>| and increase the general CPU utilization on the Internet.
>
> Yes, we lack good countermeasures.

I think the CPU concern is misplaced. We do not need to do full encryption /
decryption (which will be CPU intensive) to avoid spoofing. The worst
case CPU required is a hash on a packet, which is really no more
CPU than already needed to process a DNSSEC query/answer. This could
either be done by DNSSEC itself, by a mechanism like signing (e.g. a hash
of the answer with a preshared key), or by a mechanism like IPsec AH
transport integrity protection which is no worse (i.e. hashing the
transport layer too). There are several possibilities involving
existing protocols and potential new protocols but none seems to have
particularly serious CPU utilisation ramifications.

Alex

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On Tue, Aug 05, 2008 at 09:25:49AM +0100, Alex Bligh wrote:
> The read I took from Bert's calculations (which I think is different
> from the read Bert took) was:
> * Brute forcing the calculations shows that there is still a risk with
>  port randomisation
> * The situation is even worse if NAT is involved

We agree fully on the above. I do think that we've raised the bar beyond the
obvious. I know several people trying to spoof a SPR-nameserver in their own
networks and nobody has succeeded so far, mostly for practical reasons.

See http://tservice.net.ru/~s0mbre/blog/devel/networking/dns/index.html for
an attempt in progress involving 250-300kpps. 

> (...)
> These leads me to believe that port randomisation is insufficient as
> a solution. I believe the extra tweaks (canary ports etc.) are just
> as likely to lead to DoS vectors as improved security.

Your belief may well be correct - but I also believe that if we really apply
our minds to it, it may be possible to discover and implement simple
countermeasures that make spoofing a fully source port randomised nameserver
so hard that it becomes harder than other attacks which would lead to the
same result.

For one thing, the canary ports don't work behind a stateful firewall
without further smartness being applied. So more thinking is definitely
needed.

> >| The problems with these two techniques is that they imply a certain overhead
> >| and increase the general CPU utilization on the Internet.
> >
> >Yes, we lack good countermeasures.
> 
> I think the CPU concern is misplaced. We do not need to do full encryption /
> decryption (which will be CPU intensive) to avoid spoofing. The worst

The CPU concern is regarding the mere use of TCP or repeating queries. The
bar is set that low. I'm not sure if I agree with this sentiment btw - there
is not a lot that can be implemented without increasing packet size or
count.

	Bert

-- 
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http://netherlabs.nl              Open and Closed source services

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 =?utf-8?B?56We5piO6YGU5ZOJJ3M=?= message of "Mon, 04 Aug 2008 15:07:48
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* JINMEI Tatuya / =E7=A5=9E=E6=98=8E=E9=81=94=E5=93=89:

> My understanding is that the name server is expected to set the
> IPV6_USE_MIN_MTU socket option (when available) for its AF_INET6 UDP
> sockets.  See RFC3542 for this option.  BIND9 does that; unbound also
> seems to do so according to a quick naive grep.

Ah, thanks.  This socket option was introduced in Linux 2.6.14
(released in October 2005), so it's probably not universally
available.  (I'm not saying that the Linux kernel is the univeral
measure, but if it's not there, several other vendors probably lack
it, too.)

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=C3=9Fe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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Date: Tue, 05 Aug 2008 11:18:59 +0100
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To: bert hubert <bert.hubert@netherlabs.nl>
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--On 5 August 2008 10:38:54 +0200 bert hubert <bert.hubert@netherlabs.nl> 
wrote:

> Your belief may well be correct - but I also believe that if we really
> apply our minds to it, it may be possible to discover and implement simple
> countermeasures that make spoofing a fully source port randomised
> nameserver so hard that it becomes harder than other attacks which would
> lead to the same result.

Sure. Personally I think solutions based on limiting the trust given to
the spoofed records supplied (as I think Masataka Ohta suggested) is
the most fruitful route here (which would kill the attack dead) but I
recognise I don't have sufficient protocol guru qualifications to help
much beyond pointing out it might well require caching more than one
instance of (purportedly) the same glue record, i.e. the query which
resulted in the cache entry is going to end up forming part of the
key in the cache lookup, which is a bit of change.

Alex

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From: =?iso-8859-1?Q?=D3lafur?= =?iso-8859-1?Q?_Gu=F0mundsson?= /DNSEXT 
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Please comment if you see any mistakes,
	thanks
	Olafur


		       IETF 72, Dublin, Ireland
			      DNSEXT WG Minutes (draft)
			by Lars-Johan Liman
			edited by Olafur Gudmundsson

Chairs: Olafur Gudmundsson (OG), Andrew Sullivan (AS)

On request from the chairs, there are rough time stamps in the left
margin for when actions happened, for reference to jabber and audio
recording. Note that the jabber log is in (+0000).

Full Jabber log:
      http://jabber.ietf.org/logs/dnsext/2008-07-31.txt

[AC ...] indicates an action on someone.

AGENDA

	   Agenda for the meeting of the DNS Extensions Working Group
	   IETF 72
	   Dublin, IE		2008-07-31 1300 h (+0100) Ballroom 1

	   1.  Minute and Jabber scribes (2 min)

	   2.  Note Well (2 min)

	   3.  WG status

	       3.1 Drafts published (1 min)
	       3.2 IESG processing:

		   a.  draft-ietf-dnsext-2929bis (2 min)

	       3.3 Documents in/past WGLC

		   a.  draft-ietf-dnsext-forgery-resilience


	       3.4 Current WG Documents

		   a. draft-ietf-dnsext-dnssec-rsasha256 (8 min)
		   b. draft-ietf-dnsext-rfc2672bis-dname (8 min)
		   c. draft-ietf-dnsext-dnssec-bis-updates (10 min)
		       - discuss clarification on TA handling
		   d. draft-ietf-dnsext-rfc2671bis-edns0 (1 min)
		   e. draft-ietf-dnsext-tsig-md5-deprecated (8 min)
		       - discuss proposal for alternate text
		   f. draft-ietf-dnsext-axfr-clarify (8 min)


	       3.5 Expired WG Documents

		   a. draft-ietf-dnsext-dns-protocol-profile (5 min)

	   4.  Proposed WG work

	       4.1 draft-crocker-dnssec-algo-signal (5 min)
	       4.2 draft-vixie-dnsext-dns0x20 (see below)
	       4.3 Clarification to RFC 1123 (5 min)
	       4.4 dynamic zones and DNSSEC (M. Andrews) (5 min)
	       4.5 Warning: stuff coming because of NAT-PT

	   5.  Discussion: further forgery resilience work (30 min)

	       5.1 draft-ietf-dnsext-forgery-resilience
	       5.2 draft-vixie-dnsext-dns0x20
	       5.3 other suggestions

	   6.  A.O.B

	   7.  Close


MINUTES

1.  Minute and Jabber scribes

	Lars-Johan Liman was appointed as minute scribe, and Matthijs
	Mekking as the jabber scribe.

2.  Note Well

	The participants were made aware of the IETF "NOTE WELL"
	statement.

3.  WG status

3.1 Drafts published

	There were no new drafts published since the last meeting.

  3.2 IESG processing:

    a. draft-ietf-dnsext-2929bis

	OG reported that this document now has cleared the IESG
	"discuss" status.

  3.3 Documents in/past WGLC

   a. draft-ietf-dnsext-forgery-resilience

	OG reported that it has passed last call (LC) and that a new
	version went up this morning. The WG members were advised to
	make sure their LC issues were addressed.

3.4 Current WG Documents

   a. draft-ietf-dnsext-dnssec-rsasha256
   http://www.ietf.org/proceedings/08jul/slides/dnsext-0.pdf
	Wouter Wijngards (WW) presented (see slides). There were no
	comments. It was noted that version -05 of the document is
	out, and the WG was asked to use that for LC comments.

13:08
[AC 72.1] Andrew Sullivan to send out LC a week from today.

   b. draft-ietf-dnsext-rfc2672bis-dname
   http://www.ietf.org/proceedings/08jul/slides/dnsext-1.pdf
	WW presented (see slides).

13:13
[AC 72.2] The chairs to send this document to LC "real soon
	now". Comments on the mailing list between now and the LC will
	be treated as "LC comments".

   c. draft-ietf-dnsext-dnssec-bis-updates
      - discuss clarification on TA handling

	OG: Want to come to conclusion in sept. If the editor is
	comfortable, then the document will be sent to LC, but at
	least consensus on the list.

[AC 72.3] Andrew Sullivan to create a discussion thread for this on
     	  the list.

   d. draft-ietf-dnsext-rfc2671bis-edns0

	The editor claims that this document is done.

13:19
[AC 72.4] Olafur Gudmundsson to send the document to LC when the
     	  previous document LC ends.

   e. draft-ietf-dnsext-tsig-md5-deprecated
      - discuss proposal for alternate text

	Francis Dupont (FD) requested that the text should say "no
	longer required" rathern than "deprecated".

	Peter Koch (PK) noted that there is no good place to record
	requirement levels. That fact needs to be sorted
	out. Therefore the document is not ready for LC, even if the
	document as such is OK. We need to modify registry to contain
	that type of information.

13:25
[AC 72.5] Peter Koch to send text regarding requirement levels in the
     	  registry.

   f. draft-ietf-dnsext-axfr-clarify
   http://www.ietf.org/proceedings/08jul/slides/dnsext-5.pdf

	Ed Lewis (EL) presented and went through history. It has been
	stuck in "AD has issues" for a long time. Ed is trawling
	through the archives to find and resolve all issues.

	Dan Bernstein has raised issues in the past, Andreas
	Gustafsson (previous editor) has addressed most of them. EL
	has also checked with 4 implementors that the document doesn't
	create problems for them.

	The discussion veered into whether the master server or the
	slave server has the "right" to remove incorrect zone data
	from the zone.

	It was specifically noted that the document needs a section on
	the differences between loading a zone into a master, and
	transferring a zone in a zone transfer.

[AC 72.6] Ed Lewis to write a scratch proposal on text to address this
     	  issue, and send it to the list for discussion.

13:40
	PK: There are similar issue with root priming. There is
	possibly a difference btw. what's transferred in a zone
	transfer, and what is actually is served out in responses to
	queries.

13:44
[AC 72.7] The issue was referred to discussion on the mailing list.

	It was established that transfer of single RR messages is OK,
	and that it does not conflict with the statement in earlier
	RFCs that only "complete RR sets" shall be served in responses.

3.5 Expired WG Documents

   a. draft-ietf-dnsext-dns-protocol-profile

	Nothing has happened with this document. The chairs have
	discussed with the editors and arrived at the following: If
	this document has not started to move at the end of September,
	the chairs will kill the document.

13:52

4.  Proposed WG work

4.1 draft-crocker-dnssec-algo-signal

	Scott Rose presented. Asked the audience to please
	read, comment. Note that the document has two goals: a) to
	reduce the response size between a resolver and an
	authoritative server; and b) to signal when new algorithms are
	deployed.

[AC 72.8] Scott Rose to send request to mailing list and ask the WG to
     	  adopt the document.

4.2 draft-vixie-dnsext-dns0x20

	Discussion was deferred to agenda point 5.

4.3 Clarification to RFC 1123
     http://www.ietf.org/proceedings/08jul/slides/dnsext-3.pdf

	TLD labels are always alphabetic per RFC 1123. That needs to
	be updated. One reason is the use of internationalized domain
	names in top level domains.

	Matt Larson & Lars-Johan Liman have volunteered to draft text.

	Warnings were conveyed that there are issues both in the
	protocol specification and in registration procedures (which
	really belong with the IANA). It was also noted that old
	implementation may have problems accommodating TLDs that don't
	follow the old spec.

	Alfred Hoenes noted that there is also a problem with
	formal specifications of DNS labels, which often differ from
	document to document.

	AS noted that the update cannot be an errata, since the issue
	came up due to an errata! :-)

14:02
[AC 72.9] Matt Larson and Lars-Johan Liman to draft and post new document.

4.4 Dynamic zones and DNSSEC (M. Andrews)

	Presentation by Mark Andrews (MA). MA is looking for group of
	people to work on this, and investigate the problems.

	EL noted that he had written something up once and was willing
	to contribute it to the discussion.

14:12
	WG members were encouraged to contact MA off list if they are
	interested in working with this.

4.5 Warning: stuff coming because of NAT-PT

	OG gave a "heads-up" and asked the WG members to watch other
	WGs, and to speak up early if problems are found, since it is
	much easier to fix problems that are discovered at an early
	stage.

5.  Discussion: further forgery resilience work
     http://www.ietf.org/proceedings/08jul/slides/dnsext-6.ppt
	OG made some initial remarks regarding resilience, and urged
	the audience to deploy draft-ietf-dnsext-forgery-resilience
	without delay, even though it has just passed WGLC.

5.1 draft-ietf-dnsext-forgery-resilience
5.2 draft-vixie-dnsext-dns0x20
5.3 other suggestions
     http://www.ietf.org/proceedings/08jul/slides/dnsext-2.pdf
	WW acted as a proxy for the author and presented the dns0x20
	draft. It is noted that most server implementations echo the
	query string back to the client verbatim, so this can be
	implemented "immediately".

[Here the minute taker queued at the microphone for a while, and notes
were graciously taken by Rob Austein for the duration.]

	It was noted by the audience that the length of the query name
	makes a difference, but that the client always poses the
	"full" query to a server, and that the referral may be
	shorter, but that is irrelevant.

[Minute taker back.]

	It was noted that we only have seen very few proposals in
	documents, and that the decision on whether we want to adopt
	documents or not should be deferred until we have seen more
	proposals.

14:55

	OG urged people with good ideas to send them in as drafts, and
	requested that they be sent is as personal submissions, but
	tagged with "dnsext" to identify them as possible future WG
	work items.

[AC 72.9] Chairs will not propose the adoption of any particular work
        or collection of work until after the details of the attack is
        officially known and the WG has had time to form an opinion
        what is appropriate response.

6.  A.O.B


14:56
	John Dickinson made a short demonstration of a proof of
	concept program that infected a cache, which, in a very
	limited environment, succeeded in a matter of seconds.

7.  Close

	The meeting was adjourned.

15:01

[END]


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Ólafur Guðmundsson /DNSEXT chair wrote:
> 4.5 Warning: stuff coming because of NAT-PT
> 
>     OG gave a "heads-up" and asked the WG members to watch other
>     WGs, and to speak up early if problems are found, since it is
>     much easier to fix problems that are discovered at an early
>     stage.

Could you expand on this slightly for those of us that weren't there?

-- 
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doesn't mind who gets the credit." - Robert Woodruff

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From: Andrew Sullivan <ajs@commandprompt.com>
To: namedroppers@ops.ietf.org
Subject: Re: IETF-72 DNSEXT draft minutes
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On Tue, Aug 05, 2008 at 03:43:45PM +0100, Ben Laurie wrote:

>> 4.5 Warning: stuff coming because of NAT-PT
>>
>>     OG gave a "heads-up" and asked the WG members to watch other
>>     WGs, and to speak up early if problems are found, since it is
>>     much easier to fix problems that are discovered at an early
>>     stage.
>
> Could you expand on this slightly for those of us that weren't there?

Unfortunately, no.  We know that there is work likely to need review
as a result of NAT-PT or other, similar work being done to aid IPv6
deployment.  What we don't know exactly is what the drafts will look
like, where exactly the "home" group of these things will be, &c.
Partly, that's because I have not (and I don't believe Olafur has) had
time to review every document in this space.  But our AD has drawn our
attention to some of that work, so it seemed wise to warn everyone in
the working group that something was going to show up.

Best,

A

-- 
Andrew Sullivan
ajs@commandprompt.com
+1 503 667 4564 x104
http://www.commandprompt.com/

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From owner-namedroppers@ops.ietf.org  Tue Aug  5 11:33:55 2008
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From:	 JINMEI Tatuya / =?ISO-2022-JP?B?GyRCP0BMQEMjOkgbKEI=?=
 <Jinmei_Tatuya@isc.org>
To:	 Florian Weimer <fweimer@bfk.de>
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Subject: Re: Large EDNS0 buffer sizes and IPv6
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At Tue, 05 Aug 2008 10:49:29 +0200,
Florian Weimer <fweimer@bfk.de> wrote:

> > My understanding is that the name server is expected to set the
> > IPV6_USE_MIN_MTU socket option (when available) for its AF_INET6 UDP
> > sockets.  See RFC3542 for this option.  BIND9 does that; unbound also
> > seems to do so according to a quick naive grep.
> 
> Ah, thanks.  This socket option was introduced in Linux 2.6.14
> (released in October 2005), so it's probably not universally
> available.  (I'm not saying that the Linux kernel is the univeral
> measure, but if it's not there, several other vendors probably lack
> it, too.)

I have no doubt that some vendors lack it (e.g., Microsoft doesn't
implement it as far as I know), but referring to Linux in this context
could actually be misleading; the Linux IPv6 protocol stack (including
socket API extensions) had been a cretaceous relic largely behind many
other OSes, until the USAGI project incorporated their effort to the
mainline kernel.

---
JINMEI, Tatuya
Internet Systems Consortium, Inc.

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From owner-namedroppers@ops.ietf.org  Wed Aug  6 00:43:36 2008
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Subject: Re: correction! Re: The math of RFC3833.2.2-spoofing a randomising
 source port resolver
References: <20080801124038.GA5994@outpost.ds9a.nl> <20080804104502.GA32568@outpost.ds9a.nl> <4896FA14.2030103@necom830.hpcl.titech.ac.jp> <82hca0khmq.fsf@mid.bfk.de> <18763.1217859761@nsa.vix.com> <48976E0A.7020603@necom830.hpcl.titech.ac.jp> <68656.1217885936@nsa.vix.com>  <4898C830.9040905@necom830.hpcl.titech.ac.jp> <56305.1217978024@nsa.vix.com>
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Paul Vixie wrote:

>>>i'm comfortable with that approach, although i think it's safe to use
>>>it as glue for any NS RR,
>>
>>It is unsafe, because, 1.2.3.4 will give you forged answer for other
>>queries to ns.example2.com.
 
> when we last discussed this, i said that no nameserver should hand out
> glue for zones outside its apex, and that if it does hand out such glue
> then it ought not be believed.

As long as glue is used as glue and no other purposes, which is
necessary now, there is no point to avoid any glue information.

> my position hasn't changed.  has yours?

You should change your posision now.

BTW, the following senario seemingly require handling of additional
As so that "apex" is not a meaningful concept.

	1) an attacker ask a victim nameserver NS of example.com.

	2) the attacker repeatedly ask a victim nameserver MX of
	<random>.example.com.

	3) the victim nameserver forward the question to NS of
	example.com

	4) the attacker guess ID and gives false answers with source
	address of NS of example.com:

		<random>.example.com	MX	0 www.example.com

	with a additional record of

		www.example.com		A	<forged IP>

That is, except for glue-A, an additional record should be accepted only
if its name exactly matches the query name.

							Masataka Ohta


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From owner-namedroppers@ops.ietf.org  Wed Aug  6 00:58:39 2008
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* JINMEI Tatuya / =E7=A5=9E=E6=98=8E=E9=81=94=E5=93=89:

> I have no doubt that some vendors lack it (e.g., Microsoft doesn't
> implement it as far as I know), but referring to Linux in this context
> could actually be misleading; the Linux IPv6 protocol stack (including
> socket API extensions) had been a cretaceous relic largely behind many
> other OSes, until the USAGI project incorporated their effort to the
> mainline kernel.

Okay.  If my stack lacks it, what should I cap the EDNS0 buffer size
to?  1232 (1280 minues 40 minus 8)? 1200?

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=C3=9Fe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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Cc: Paul Vixie <vixie@isc.org>,  namedroppers@ops.ietf.org
Subject: Re: correction! Re: The math of RFC3833.2.2-spoofing a randomising source port resolver
References: <20080801124038.GA5994@outpost.ds9a.nl>
	<20080804104502.GA32568@outpost.ds9a.nl>
	<4896FA14.2030103@necom830.hpcl.titech.ac.jp>
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From: Florian Weimer <fweimer@bfk.de>
Date: Wed, 06 Aug 2008 10:55:36 +0200
In-Reply-To: <48995430.6040306@necom830.hpcl.titech.ac.jp> (Masataka Ohta's message of "Wed, 06 Aug 2008 16:35:12 +0900")
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* Masataka Ohta:

> That is, except for glue-A, an additional record should be accepted only
> if its name exactly matches the query name.

This is correct.

Additional section processing has been useless for a while.  It turns
out that it is very difficult to make use of data in the additional
section in a dual stack environment because lack of A (or AAAA) RRs in
the additional section for a MX DNAME does not mean that these records
do not exist in DNS.  Consequently, you need to perform an additional
DNS transaction anyway in many cases.

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=DFe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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On Wed, 6 Aug 2008, Masataka Ohta wrote:
> Paul Vixie wrote:

> > will you propose text for the forgery-resilience draft that expresses
> > your point of view?
>
> "Glue A from a name server is, in general, outside of the zone served
> by the name server and is never authoritative. The glue can be used
> only for the original query."

Shouldn't this kind of thing go in a revision of RFC 2181?

Tony.
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-----BEGIN PGP SIGNED MESSAGE-----
Hash: SHA1

JINMEI Tatuya / ç¥žæ˜Žé�”å“‰ wrote:
| At Mon, 04 Aug 2008 15:07:48 -0700,
| JINMEI Tatuya <Jinmei_Tatuya@isc.org> wrote:
|
|>> Apparently, this was raised by Itojun at IETF48 back in 2000, but I
|>> don't see how it was resolved.  Implementations with buffer sizes
|>> greater than 1400 bytes seem to fragment according to the link MTU
|>> they are connected to, and do not care about the path MTU.  (I haven't
|>> got native IPv6, so it's hard for me to tell what's going on.)
|> My understanding is that the name server is expected to set the
|> IPV6_USE_MIN_MTU socket option (when available) for its AF_INET6 UDP
|> sockets.  See RFC3542 for this option.  BIND9 does that; unbound also
|> seems to do so according to a quick naive grep.
|
| In this context I should have rather focused on authoritative
| servers...for that matter, NSD also seems to do so according to a
| quick naive grep.

Yes, NSD does this:
If MIN_MTU option exists - sets that option.
Else set the edns bufsize to the IPV6_MIN_MTU

Best regards,
~   Wouter
-----BEGIN PGP SIGNATURE-----
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Comment: Using GnuPG with Fedora - http://enigmail.mozdev.org

iEYEARECAAYFAkiZrw0ACgkQkDLqNwOhpPjYmQCggZLzbpH7KSIkw6clsP42g37u
u/IAnA93Ulwi56wvW/vkljRy9idG/uBO
=oy48
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> > > will you propose text for the forgery-resilience draft that expresses
> > > your point of view?
> >
> > "Glue A from a name server is, in general, outside of the zone served
> > by the name server and is never authoritative. The glue can be used
> > only for the original query."
> 
> Shouldn't this kind of thing go in a revision of RFC 2181?

not that text, certainly.  but i do agree in general that once we can agree
on what should be done, an update to RFC 2181 and 2308 should be made.

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From owner-namedroppers@ops.ietf.org  Wed Aug  6 09:19:21 2008
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This idea is probably even uglier than the 0x20 draft. :-)

Begin forwarded message:

> From: IETF I-D Submission Tool <idsubmission@ietf.org>
> Date: August 6, 2008 15:46:00 BST
> To: jim@rfc1035.org
> Subject: New Version Notification for draft-reid-dnsext-aleatoric-00
>
>
> A new version of I-D, draft-reid-dnsext-aleatoric-00.txt has been  
> successfuly submitted by Jim Reid and posted to the IETF repository.
>
> Filename:	 draft-reid-dnsext-aleatoric
> Revision:	 00
> Title:		 A DNS Resource Record for Additional Entropy
> Creation_date:	 2008-08-06
> WG ID:		 Independent Submission
> Number_of_pages: 14
>
> Abstract:
> A scheme to defend against cache poisoning attacks against the Domain
> Name System (DNS) by predicting the ID and source port number of
> outgoing queries is described in this draft.  It proposes a new
> resource record to provide a mechanism to introduce additional
> entropy into DNS queries.
>
>
>
> The IETF Secretariat.
>
>


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> > my position hasn't changed.  has yours?
> 
> You should change your posision now.

that's what you said ten years ago, too.  let me caution you now, as then,
against any attempt at "proof by vigorous reassertion."  i've demonstrated
(again) that your proposed solution is more complex than what everybody now
does (which is to either not send or not accept out-of-baliwick glue) and
that your proposed solution creates some new problems while failing to fully
address the problem we have now.  what's your factual, detailed, response?

> BTW, the following senario seemingly require handling of additional
> As so that "apex" is not a meaningful concept.
> 
> 	1) an attacker ask a victim nameserver NS of example.com.
> 
> 	2) the attacker repeatedly ask a victim nameserver MX of
> 	<random>.example.com.
> 
> 	3) the victim nameserver forward the question to NS of
> 	example.com
> 
> 	4) the attacker guess ID and gives false answers with source
> 	address of NS of example.com:
> 
> 		<random>.example.com	MX	0 www.example.com
> 
> 	with a additional record of
> 
> 		www.example.com		A	<forged IP>
> 
> That is, except for glue-A, an additional record should be accepted only
> if its name exactly matches the query name.
> 
> 							Masataka Ohta

i agree with florian's answer to this, where he said that the additional
data section is mostly useless.  i agree with your proposed policy, as
stated above.  the only A or AAAA RRs that should be sent or accepted in
the additional data section are those which (a) referenced by an NS RR
in the authority or answer sections, and (b) having owner names at or below
the owner name of the NS RRset who references them.  these records should
be sent onward if the NS RRset which references them is sent onward.  these
records should be used by the iterator to reach the nameservers whose 
addresses they are.  they should not be used in any other way, and if some
other use is demanded, then normal recursion should be done to get real
answers to replace what's in cache before that use is made.

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From:	 JINMEI Tatuya / =?ISO-2022-JP?B?GyRCP0BMQEMjOkgbKEI=?=
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At Wed, 06 Aug 2008 09:50:30 +0200,
Florian Weimer <fweimer@bfk.de> wrote:

> > I have no doubt that some vendors lack it (e.g., Microsoft doesn't
> > implement it as far as I know), but referring to Linux in this context
> > could actually be misleading; the Linux IPv6 protocol stack (including
> > socket API extensions) had been a cretaceous relic largely behind many
> > other OSes, until the USAGI project incorporated their effort to the
> > mainline kernel.
> 
> Okay.  If my stack lacks it, what should I cap the EDNS0 buffer size
> to?  1232 (1280 minues 40 minus 8)? 1200?

I don't think the EDNS0 buffer size matters in this context: it's the
receiver's (=client's) buffer size, while it's the sender that needs
(or has to deal with the case with missing) IPV6_USE_MIN_MTU.  Or are
you talking about something like BIND9's specific feature
"max-udp-size"?  If so, I'd say it should be not larger than 1232 (if
there's any possibility that some extension headers can be inserted to
DNS responses, it should be smaller accordingly).

---
JINMEI, Tatuya
Internet Systems Consortium, Inc.

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From owner-namedroppers@ops.ietf.org  Wed Aug  6 17:55:44 2008
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Paul Vixie wrote:

>>>my position hasn't changed.  has yours?
>>
>>You should change your posision now.

> that's what you said ten years ago, too.  let me caution you now, as then,
> against any attempt at "proof by vigorous reassertion."

The bitter reality for you is that, if you admitted your mistake 10 years
ago, Kaminsky couldn't have used glue-A for his attack.

Kaminsky's originality beyond rfc3833 is to have provided a yet another
proof that your authority model is broken.

> i've demonstrated
> (again) that your proposed solution is more complex than what everybody now
> does

That many people are using a broken authority model means they
are insecure.

> i agree with florian's answer to this, where he said that the additional
> data section is mostly useless.  i agree with your proposed policy, as
> stated above.  the only A or AAAA RRs that should be sent or accepted in
> the additional data section are those which (a) referenced by an NS RR
> in the authority or answer sections, and (b) having owner names at or below
> the owner name of the NS RRset who references them.

Totally wrong. I never proposed such a broken policy.

							Masataka Ohta


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Florian Weimer wrote:

> Or you cache referrals without storing any name server name.
> Conceptually, this seems to be the much simpler approach.

If you mean the cached referral is tagged with the original query,
the complexity is no different from mine.

If you don't, it's insecure.

Paul Vixie wrote:

> i don't think so, since nameservers can be renumbered without being
> renamed.

TTL, which must be properly configured by zone administrators, takes
care of it.

						Masataka Ohta


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> From: Masataka Ohta <mohta@necom830.hpcl.titech.ac.jp>
> 
> The bitter reality for you is that, if you admitted your mistake 10 years
> ago, Kaminsky couldn't have used glue-A for his attack.

kaminsky's initial vector was poisoned NS RRsets, so, i doubt that i would
have seen myself as culpable in that way, even if i thought i'd made the
mistake you think i made.

> Kaminsky's originality beyond rfc3833 is to have provided a yet another
> proof that your authority model is broken.

that explaination is just not detailed or complete enough.  please try again?

> That many people are using a broken authority model means they
> are insecure.

that explaination is just not detailed or complete enough.  please try again?

> > i agree with florian's answer to this, where he said that the additional
> > data section is mostly useless.  i agree with your proposed policy, as
> > stated above.  the only A or AAAA RRs that should be sent or accepted in
> > the additional data section are those which (a) referenced by an NS RR
> > in the authority or answer sections, and (b) having owner names at or below
> > the owner name of the NS RRset who references them.
> 
> Totally wrong. I never proposed such a broken policy.
> 
> 							Masataka Ohta

i was agreeing with what you had stated above, and then explaining how i
related this policy change to my own.  i think if you read my words
carefully you will see that we are not so far apart.

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bert hubert wrote:

> How about just not caching the glue-A?

If you receive a referral and try several nameservers, you must
keep the glue information, which is called caching.

> It is out of bailiwick.

As I showed with MX, under ID guessing attack, "bailiwick" is a
broken concept.

Throw it away.

						Masataka Ohta


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Date: Thu, 07 Aug 2008 10:14:42 +0900
From: Masataka Ohta <mohta@necom830.hpcl.titech.ac.jp>
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Paul Vixie wrote:

>>Kaminsky's originality beyond rfc3833 is to have provided a yet another
>>proof that your authority model is broken.

> that explaination is just not detailed or complete enough.  please try again?

The bitter reality for you is that, if you admitted your mistake 10
years ago, Kaminsky couldn't have used glue-A for his attack.

>>That many people are using a broken authority model means they
>>are insecure.

> that explaination is just not detailed or complete enough.  please try again?

The bitter reality for people using a broken authority model is that,
if they admitted their mistake 10 years ago, Kaminsky couldn't have
used glue-A for his attack.

> i was agreeing with what you had stated above, and then explaining how i
> related this policy change to my own.  i think if you read my words
> carefully you will see that we are not so far apart.

First, you must forget broken concepts such as apex and bailiwick.

Then, you must read my words carefully.

> That is, except for glue-A, an additional record should be accepted only
> if its name exactly matches the query name.

						Masastaka Ohta


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masataka, i think we're done here.  i have treated you respectfully, as one
internet engineer to another, and you have responded without honour.  goodbye.
--paul

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Paul Vixie wrote:

> masataka, i think we're done here.

No. You have been done 10 years ago.

						Masataka Ohta



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-----BEGIN PGP SIGNED MESSAGE-----
Hash: SHA1

Hi,

A new version of my resolver (Unbound) with additional filtering of
responses to counter the recently disclosed vulnerability at blackhat
was just released. This filtering is in addition to the bailiwick
checking. I would like to say what I did, here, because this is easy to
do, and effective against certain types of 'the Kaminsky attack'.

1) Stuff in the additional section. RFC2181. Understand why Masataka and
Paul think it is very important, and worth bickering over. Just mentioning.

2) CNAME chains.  The first CNAME, that starts with the query name, is
OK. Everything after that, especially if in-bailiwick and giving nice
hints about www.example.com and so on is ignored from incoming messages.
Instead, the target of the CNAME is queried again. I think BIND already
does this.

3) DNAMEs. Unvalidated DNAMEs are not used from the cache. I believe
BIND also does this already.  Thus, a new request is done for every
query under a (not DNSSEC validated) DNAME, receiving a new redirection
for that one query.

So, only stuff that exactly matches the query is left in the answer
section.  The rest is ignored (basically, I delete it immediately).

This simply rejects a couple of loopholes without great additional
complexity or bother. It does not protect fully against 'The Kaminsky
Attack', only some variations are stopped.

The best solution is of course DNSSEC. Crypto signatures instead of
randomisation games. Enable DNSSEC validation now.

Best regards,
~   Wouter

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 06:49:09 2008
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Date: Thu, 7 Aug 2008 15:42:37 +0200
From: bert hubert <bert.hubert@netherlabs.nl>
To: Namedroppers <namedroppers@ops.ietf.org>
Subject: OFFTOPIC: DNSSEC groupthink versus improving DNS
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On Thu, Aug 07, 2008 at 01:00:51PM +0200, Wouter Wijngaards wrote:
> The best solution is of course DNSSEC. Crypto signatures instead of
> randomisation games. Enable DNSSEC validation now.

Not specifically aimed at you Wouter, but it appears the most vocal people
in the DNS world are starting to suffer from "groupthink". 

http://en.wikipedia.org/wiki/Groupthink

"A mode of thinking that people engage in when they are deeply involved in a
 cohesive in-group, when the members' strivings for unanimity override their
 motivation to realistically appraise alternative courses of action"

"Groupthink tends to occur on committees and in large organizations. 
 [..]"

For a fine compendium of the kind of statements I mean, please see
http://www.dnssec-deployment.org/news/dnssecthismonth/current/

	DNSSEC cited as "only full solution" to recent DNS vulnerability

	"DNSSEC is the only full solution."

	"We at ISC hope that this issue will draw attention to DNSSEC, which
	in the end will only be the real solution"

And this can't be good - it is leading us to make statements which are
patently untrue, like "turn on DNSSEC to be safe".

Or 79 page presentations called "DNSSEC in six minutes" - giving people 4.6
seconds per page. It is just not real.
http://www.isc.org/sw/bind/docs/DNSSEC_in_6_minutes.pdf 

Or asking people repeatedly to remove the phrase "under development" when
DNSSEC is referred to as a solution under development - which it patently
is. 

If the goal is to deploy DNSSEC quickly, roll out the tools surrounding it,
invent the protocols for getting your keying material upstream, widen the
registry-registrar protocols to fit these records, create the emergency key
rollover procedures (and don't hide the need for them), implement 'auto-sign
yes;' etc etc etc. The only way DNSSEC will ever work if it is only slightly
harder to operate than DNS.

But if you care about DNSSEC, please stop pretending DNSSEC is ready to
deploy and just waiting for people to get around to it.

If you care about DNSSEC, don't hide that it might in itself have security
implications.

If you care about DNSSEC, please also stop pretending it is not far harder
to operate than DNS itself. DNS is already considered to be difficult, and
operators mess it up all the time. It is not like adding an 's' to
'http://'.

All these things will come back to haunt you when people actually do follow
the advice to turn on DNSSEC now, and discover they've either done something
that doesn't help (signing without getting the trust anchor used), or have
actually caused their domains to go down, because they did not
institutionalize the key rollover procedures.

("You mean this goes down if I don't re-sign in time? Wow!").

The reason I rant on about this is that I care deeply about DNS, and that
DNS is *currently* under attack. While DNSSEC is agressively branded as a
fine solution, at best, it will be a solution in a few years.

Additionally, given things I've said before, I personally don't think DNSSEC
will ever see wide usage in the real world, so I feel very strongly that not
only do we need to improve DNS in the short term, the short term solution
also needs to be the long term solution.

But no matter what I feel - please everybody take a minute to read the
symptoms of groupthink, and wonder if we are still doing the best job we can
to improve DNS in the real world. 

Because that is our goal. I hope. 

	Bert

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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bert hubert wrote:
> Or 79 page presentations called "DNSSEC in six minutes" - giving people 4.6
> seconds per page. It is just not real.
> http://www.isc.org/sw/bind/docs/DNSSEC_in_6_minutes.pdf 

I've seen this document in the past and it actually turned me and others
completely off the idea of DNSSEC, which in part was what led to me
playing with encryption funnily enough, because it seems to me most are
promoting 30 day TTLs on the sigs, which means 30 days of replay attacks
potentially, not to mention the whole re-signing every 30 days.

Who ever thought that does not live in the real world, people
administering servers with X.509 certs that expire yearly is bad enough,
but every 30 days or less???

That alone is going to be a show stopped for most if not all admins with
too many things to do and not enough time to do everything.

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 08:31:19 2008
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From: Paul Vixie <vixie@isc.org>
To: Wouter Wijngaards <wouter@NLnetLabs.nl>
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> 1) Stuff in the additional section. RFC2181. Understand why Masataka and
> Paul think it is very important, and worth bickering over. Just mentioning.

first, we should not send, or if we receive, we should not cache or forward,
anything in the additional section that could be found using a new query.
this rules out all records except those referred to by NS RRs in an authority
or answer section, whose target names are at-or-below the NS RR owner name.

second, use these "glue" records only when trying to reach these nameservers,
or when answering questions or sending referrals about these nameservers.  do
not use them in answer sections, nor as additional data for MX or SRV or any
other purpose.  if needed for such "other purpose", go fetch them normally.

the small technical differences that masataka and i were bickering over have
to do with implicit antialiasing, and circular nonreachability.  i'll explain
for the gallery, even though i do not think that masataka will hear me.  if
the following responses are heard:

	authority	foo.org		NS     ns1.a.foo.org
	additional	ns1.a.foo.org	A      10.0.0.51

	authority	a.foo.org	NS     ns1.a.foo.org
	additional	ns1.a.foo.org	A      10.0.0.71

then there is a configuration error which crosses zone boundaries and is not
subject to normally operational fixits.  since both glue records are necessary
for reaching the nameserver, an RDNS has a difficult decision to make.
masataka recommends one choice, i recommend the other.  in masataka's design
the RDNS would contextualize the values of ns1.a.foo.org and use each one at
different times, depending on which NS RR was being followed.  in my design
there would never be more than one value for the glue in the rdns cache, and
it would be the deepest one (so, the one matching the most labels with the
zone whose delegation it was given for.)

then there's circular nonreachability.  in the following configuration:

	foo.org		NS	ns1.bar.net

	bar.net		NS	ns2.foo.org

my design says that neither zone is reachable, since no glue given by the
foo.org or .org servers for the ns1.bar.net nameserver would be believed,
and no glue given by the bar.net or .net servers for ns1.foo.org would be
believed.  in masataka's design, this glue can be sent, and heard, and then
used contextually, and both zones would be reachable.

these issues are now moot, since the baliwick rules of glue transmission
and reception are now enshrined in most operating nameservers as well as
several RFCs, and are "house rules" in terms of the DNSSEC design, which
contemplates baliwick issues more deeply than pre-SEC DNS did.  we can go
on bickering, and we could reopen these settled standards questions, but
we should stop treating them as open or unsettled questions.

i remain troubled and saddened by my inability to communicate effectively
with masataka, he is a brilliant and passionate dns engineer who among other
things came up with a better design for Secure DNS than any of the ones we
have standardized, and anyone who studies his work can learn a lot.  however,
our far flung rough and tumble community demands proper decorum and not just
technical excellence, and for my own self esteem i have to draw the line
someplace.

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> From: Duane <duane@e164.org>
> 
> bert hubert wrote:
> > Or 79 page presentations called "DNSSEC in six minutes" - giving people 4.6
> > seconds per page. It is just not real.
> > http://www.isc.org/sw/bind/docs/DNSSEC_in_6_minutes.pdf 
> 
> I've seen this document in the past and it actually turned me and others
> completely off the idea of DNSSEC, ...

you are both missing the point of that document.  it's not a six minute
presentation.  but after you sit through that presentation, you can get
dnssec running in six minutes.  (we've measured.)  which is not to say
that dnssec is easy -- i know that at ISC we're thinking seriously of
dedicating the whole BIND 9.7 release to dnssec tools and usability.

> ... which in part was what led to me playing with encryption funnily
> enough, because it seems to me most are promoting 30 day TTLs on the
> sigs, which means 30 days of replay attacks potentially, not to mention
> the whole re-signing every 30 days.

you can use whatever TTL you want.  but more importantly, are you saying
we should discard a protocol because of the quality of early implementations
especially in terms of usability?  because if that were true i'm pretty
sure TCP/IP should have been shot dead back in 1985 or so.  likewise X11,
BSD, Linux, Windows, and MAC/OS.

> Who ever thought that does not live in the real world, people
> administering servers with X.509 certs that expire yearly is bad enough,
> but every 30 days or less???
> 
> That alone is going to be a show stopped for most if not all admins with
> too many things to do and not enough time to do everything.

duane, i understand why bert's a dnssec denier.  but i urge you to study
the historical debates and the threat models document and think carefully
before you climb on that bandwagon.

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 09:04:45 2008
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From: Paul Vixie <vixie@isc.org>
To: bert hubert <bert.hubert@netherlabs.nl>
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> From: bert hubert <bert.hubert@netherlabs.nl>
> ...
> And this can't be good - it is leading us to make statements which are
> patently untrue, like "turn on DNSSEC to be safe".

"turn on DNSSEC so that some day we can stop fighting endless brushfires."

> But if you care about DNSSEC, please stop pretending DNSSEC is ready to
> deploy and just waiting for people to get around to it.

dnssec (the protocol) is ready to deploy.  the usability of the tools is
a bit low at the moment but that's expected in early days.

> ("You mean this goes down if I don't re-sign in time? Wow!").

BIND 9.6 will have online re-signing.  presumably others will also do this.

> But no matter what I feel - please everybody take a minute to read the
> symptoms of groupthink, and wonder if we are still doing the best job we
> can to improve DNS in the real world.
> 
> Because that is our goal. I hope. 

i'd like to avoid re-debating the need for dnssec every few weeks.  it's
been a decade and a half.  these debates are just distractions.  anyone
whose vision or business plan or past representations to customers or code
base is just not adaptable to dnssec, please simply indulge those of us
who can see a need for it and who think we know how to make it happen.


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From owner-namedroppers@ops.ietf.org  Thu Aug  7 09:21:12 2008
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Subject: RE: OFFTOPIC: DNSSEC groupthink versus improving DNS
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Hear hear !!

Jesper


> -----Original Message-----
> From: owner-namedroppers@ops.ietf.org [mailto:owner-
> namedroppers@ops.ietf.org] On Behalf Of bert hubert
> Sent: Thursday, August 07, 2008 3:43 PM
> To: Namedroppers
> Subject: OFFTOPIC: DNSSEC groupthink versus improving DNS
> 
> On Thu, Aug 07, 2008 at 01:00:51PM +0200, Wouter Wijngaards wrote:
> > The best solution is of course DNSSEC. Crypto signatures instead of
> > randomisation games. Enable DNSSEC validation now.
> 
> Not specifically aimed at you Wouter, but it appears the most vocal
> people
> in the DNS world are starting to suffer from "groupthink".
> 
> http://en.wikipedia.org/wiki/Groupthink
> 
> "A mode of thinking that people engage in when they are deeply involved
> in a
>  cohesive in-group, when the members' strivings for unanimity override
> their
>  motivation to realistically appraise alternative courses of action"
> 
> "Groupthink tends to occur on committees and in large organizations.
>  [..]"
> 
> For a fine compendium of the kind of statements I mean, please see
> http://www.dnssec-deployment.org/news/dnssecthismonth/current/
> 
> 	DNSSEC cited as "only full solution" to recent DNS vulnerability
> 
> 	"DNSSEC is the only full solution."
> 
> 	"We at ISC hope that this issue will draw attention to DNSSEC,
> which
> 	in the end will only be the real solution"
> 
> And this can't be good - it is leading us to make statements which are
> patently untrue, like "turn on DNSSEC to be safe".
> 
> Or 79 page presentations called "DNSSEC in six minutes" - giving people
> 4.6
> seconds per page. It is just not real.
> http://www.isc.org/sw/bind/docs/DNSSEC_in_6_minutes.pdf
> 
> Or asking people repeatedly to remove the phrase "under development"
> when
> DNSSEC is referred to as a solution under development - which it
> patently
> is.
> 
> If the goal is to deploy DNSSEC quickly, roll out the tools surrounding
> it,
> invent the protocols for getting your keying material upstream, widen
> the
> registry-registrar protocols to fit these records, create the emergency
> key
> rollover procedures (and don't hide the need for them), implement
> 'auto-sign
> yes;' etc etc etc. The only way DNSSEC will ever work if it is only
> slightly
> harder to operate than DNS.
> 
> But if you care about DNSSEC, please stop pretending DNSSEC is ready to
> deploy and just waiting for people to get around to it.
> 
> If you care about DNSSEC, don't hide that it might in itself have
> security
> implications.
> 
> If you care about DNSSEC, please also stop pretending it is not far
> harder
> to operate than DNS itself. DNS is already considered to be difficult,
> and
> operators mess it up all the time. It is not like adding an 's' to
> 'http://'.
> 
> All these things will come back to haunt you when people actually do
> follow
> the advice to turn on DNSSEC now, and discover they've either done
> something
> that doesn't help (signing without getting the trust anchor used), or
> have
> actually caused their domains to go down, because they did not
> institutionalize the key rollover procedures.
> 
> ("You mean this goes down if I don't re-sign in time? Wow!").
> 
> The reason I rant on about this is that I care deeply about DNS, and
> that
> DNS is *currently* under attack. While DNSSEC is agressively branded as
> a
> fine solution, at best, it will be a solution in a few years.
> 
> Additionally, given things I've said before, I personally don't think
> DNSSEC
> will ever see wide usage in the real world, so I feel very strongly
> that not
> only do we need to improve DNS in the short term, the short term
> solution
> also needs to be the long term solution.
> 
> But no matter what I feel - please everybody take a minute to read the
> symptoms of groupthink, and wonder if we are still doing the best job
> we can
> to improve DNS in the real world.
> 
> Because that is our goal. I hope.
> 
> 	Bert
> 
> --
> http://www.PowerDNS.com      Open source, database driven DNS Software
> http://netherlabs.nl              Open and Closed source services
> 
> --
> to unsubscribe send a message to namedroppers-request@ops.ietf.org with
> the word 'unsubscribe' in a single line as the message text body.
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To: Paul Vixie <vixie@isc.org>
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	Wouter Wijngaards <wouter@NLnetLabs.nl>
Subject: Re: Additional filtering of responses
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Paul Vixie wrote on 08/07/2008 05:22:32 PM:

> Re: Additional filtering of responses
> 
> > 1) Stuff in the additional section. RFC2181. Understand why Masataka 
and
> > Paul think it is very important, and worth bickering over. Just 
mentioning.
> 
> first, we should not send, or if we receive, we should not cache or 
forward,
> anything in the additional section that could be found using a new 
query.
> this rules out all records except those referred to by NS RRs in an 
authority
> or answer section, whose target names are at-or-below the NS RR owner 
name.


What does the scripture say about the following, very small (see * below) 
response:

;; ->>HEADER<<- opcode: QUERY, status: NOERROR, id: 37612
;; flags: qr aa; QUERY: 1, ANSWER: 1, AUTHORITY: 1, ADDITIONAL: 0

;; QUESTION SECTION:
;010a.example.          IN      A

;; ANSWER SECTION:
010a.example.           86400   IN      A       192.0.2.9

;; AUTHORITY SECTION:
example.                86400   IN      NS      010a.example.

;; Query time: 3 msec
;; SERVER: 192.0.2.10#53(192.0.2.10)

No glue. No additional section. 

Is the address record in the answer section cached? 
When cached, is 192.0.2.9 considered authoritative now for future lookups 
under example? 
Will that NS record ever expire if a query is send once a day ?

With all scrubbing and additional filtering of responses, will this 
response cause a successful cache-(over)write of example NS records?

No criticism about scrubbers and filters, just curious of what 
implementations do and what the protocol dictates.

Roy Arends
Nominet.

(*) The wireformat of this DNS message is just 60 octets due to the use of 
compression pointers.

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 09:52:09 2008
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From: "Roy Arends" <roy@nominet.org.uk>
> Paul Vixie wrote on 08/07/2008 05:22:32 PM:
> > ...
> 
> What does the scripture say about the following, very small (see * below) 
> response:

what am i, your prophet?  to hell with the scriptures, here's my take on it.

> ;; ->>HEADER<<- opcode: QUERY, status: NOERROR, id: 37612
> ;; flags: qr aa; QUERY: 1, ANSWER: 1, AUTHORITY: 1, ADDITIONAL: 0
> 
> ;; QUESTION SECTION:
> ;010a.example.          IN      A
> 
> ;; ANSWER SECTION:
> 010a.example.           86400   IN      A       192.0.2.9
> 
> ;; AUTHORITY SECTION:
> example.                86400   IN      NS      010a.example.
> 
> ;; Query time: 3 msec
> ;; SERVER: 192.0.2.10#53(192.0.2.10)
> 
> No glue. No additional section. 
> 
> Is the address record in the answer section cached? 

yes, since it matches the qname and it's in the zone you were querying.

> When cached, is 192.0.2.9 considered authoritative now for future lookups 
> under example? 

yes, since it was received as an answer, it's presumed to be the same as
the answer one would get by discarding it and re-asking for it.  (that's
what's different about this case vs. the additional data case.)

> Will that NS record ever expire if a query is send once a day ?

your example shows an authoritative response.  your question here is about
expiry and therefore caching.  the TTL would tick down, and on the seventh
day it would expire, and a subsequent query would cause us to go back to
the root zone for a new delegation response.

> With all scrubbing and additional filtering of responses, will this 
> response cause a successful cache-(over)write of example NS records?

yes.

> No criticism about scrubbers and filters, just curious of what 
> implementations do and what the protocol dictates.

the protocol is horribly weak in terms of datapath protection.  the whole
thing is laboratory-grade.  the only true fix for any of this is dnssec.

> Roy Arends
> Nominet.
> 
> (*) The wireformat of this DNS message is just 60 octets due to the use
> of compression pointers.

i think DW (DNS-OARC) has a wiki where stuff like this can be shared, fwiw.

note that RTT banding, to make more random the RDNS' selection of an ADNS,
is another terrible idea (similar to dns-0x20 in its terribleness but also
in the ability to deploy it without a forklift of the whole infrastructure),
which would make it little bit harder to spoof .COM delegation responses.

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 10:02:25 2008
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Date: Thu, 07 Aug 2008 12:57:00 -0400
From: Brian Dickson <briand@ca.afilias.info>
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To: Paul Vixie <vixie@isc.org>
CC: Wouter Wijngaards <wouter@NLnetLabs.nl>, 
 Namedroppers <namedroppers@ops.ietf.org>,
 dns-operations@lists.oarci.net
Subject: Forgery resilience idea - wildcard cooperative defense
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While doing some free-associating around the Kaminsky presentation, I 
began pondering wildcards.

Specifically, what could we do, using wildcards, to nip the 
$RANDOM.example.com problem in the bud?

Here's the beginnings of a meme on this concept...

If:
Authority server for example.com has a wildcard which means to 
communicate that anything matching the wildcard should get NXDOMAIN answers;
And:
A recursive resolver, upon getting an NXDOMAIN for a *specific* 
subdomain query, such as foo000001.example.com, do a query for the "*" 
literal;
Then:
The recursive resolver could cache the wildcard NXDOMAIN for $TTL, and 
immediately answer queries for all such garbage subdomains.

Then, anyone wanting to protect their domain would be able to add in the 
wildcard NXDOMAIN.

Or, plan B (which does not require any work on the part of domain 
administrators, only modified code on resolvers and authority servers):

If:
An authority server, upon receiving a query for wildcard literal "*", if 
it does not find a match, returns in the Additional section, an 
enumerated list of delegated subdomains.
And:
(same as "And" clause above)
Then:
Additional responses get cached for positive enumerated answers, and an 
additional wildcard literal "*" gets synthesized for NXDOMAIN on all 
other subdomains.

Both of these appear, at first blush, to remove the non-TTL basis for 
triggering new windows for birthday attacks, and thus can significantly 
improve the resilience to forgery attacks of the new Kaminsky vector 
variants.

Thoughts?

Brian Dickson

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To: Brian Dickson <briand@ca.afilias.info>
cc: Wouter Wijngaards <wouter@NLnetLabs.nl>,
    Namedroppers <namedroppers@ops.ietf.org>,
    dns-operations@lists.oarci.net
In-Reply-To: Your message of "Thu, 07 Aug 2008 12:57:00 -0400."
             <489B295C.3020002@ca.afilias.info> 
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Subject: Re: Forgery resilience idea - wildcard cooperative defense
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> While doing some free-associating around the Kaminsky presentation, I 
> began pondering wildcards.
> 
> Specifically, what could we do, using wildcards, to nip the 
> $RANDOM.example.com problem in the bud?
> ...

any solution requiring cooperative action/change by both the RDNS and ADNS
has a cost that's equivilent to "deploy DNSSEC".  the thing that's good
about UDP port randomization, or DNS-0x20, is that it only requires change
in one place (the RDNS in those cases, but an ADNS-only solution would also
be cheaper than "deploy DNSSEC".)

for solutions involving "upgrade all nodes", the first term of the expression
of deployment cost is in touching all those nodes, and the actual complexity
or difficulty of the new protocol is a distant second term, easily managed
through normal and inevitable capitalistic incentives.

for all solutions having the same cost as "deploy DNSSEC", compare the
expected benefits.  the DNS datapath is long and twisty and involves both
on-wire and off-wire transport.  zone storage on primary and secondary
servers, zone transfer between those servers, zone content generation from
databases, responses from ADNS to RDNS, responses from RDNS to stub, and
application to stub API, are all corruptible elements of the DNS datapath.

> Thoughts?
> 
> Brian Dickson

among all same-cost solutions, which one protects the largest amount of
the DNS datapath?  hint: it's not based on wildcards.

i would love to hear more ideas that involve only one point of action/change,
like UDP port randomization or DNS-0x20.

paul

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vixie@vix.com wrote on 08/07/2008 06:46:44 PM:

> From: "Roy Arends" <roy@nominet.org.uk>
> > Paul Vixie wrote on 08/07/2008 05:22:32 PM:
> > > ...
> > 
> > What does the scripture say about the following, very small (see * 
below) 
> > response:
> 
> what am i, your prophet?  to hell with the scriptures, here's my take on 
it.

I was trying to address the group in general, you happened to be on the 
recipient list. Forgot to scrub that ;-)

> > ;; ->>HEADER<<- opcode: QUERY, status: NOERROR, id: 37612
> > ;; flags: qr aa; QUERY: 1, ANSWER: 1, AUTHORITY: 1, ADDITIONAL: 0
> > 
> > ;; QUESTION SECTION:
> > ;010a.example.          IN      A
> > 
> > ;; ANSWER SECTION:
> > 010a.example.           86400   IN      A       192.0.2.9
> > 
> > ;; AUTHORITY SECTION:
> > example.                86400   IN      NS      010a.example.
> > 
> > ;; Query time: 3 msec
> > ;; SERVER: 192.0.2.10#53(192.0.2.10)
> > 
> > No glue. No additional section. 
> > 
> > Is the address record in the answer section cached? 
> 
> yes, since it matches the qname and it's in the zone you were querying.
> 
> > When cached, is 192.0.2.9 considered authoritative now for future 
lookups 
> > under example? 
> 
> yes, since it was received as an answer, it's presumed to be the same as
> the answer one would get by discarding it and re-asking for it.  (that's
> what's different about this case vs. the additional data case.)
> 
> > Will that NS record ever expire if a query is send once a day ?
> 
> your example shows an authoritative response.  your question here is 
about
> expiry and therefore caching.  the TTL would tick down, and on the 
seventh
> day it would expire, and a subsequent query would cause us to go back to
> the root zone for a new delegation response.
> 
> > With all scrubbing and additional filtering of responses, will this 
> > response cause a successful cache-(over)write of example NS records?
> 
> yes.
> 
> > No criticism about scrubbers and filters, just curious of what 
> > implementations do and what the protocol dictates.
> 
> the protocol is horribly weak in terms of datapath protection.  the 
whole
> thing is laboratory-grade.  the only true fix for any of this is dnssec.
> 
> > Roy Arends
> > Nominet.
> > 
> > (*) The wireformat of this DNS message is just 60 octets due to the 
use
> > of compression pointers.
> 
> i think DW (DNS-OARC) has a wiki where stuff like this can be shared, 
fwiw.

Thanks for the pointer. I'll ping DW.

> note that RTT banding, to make more random the RDNS' selection of an 
ADNS,
> is another terrible idea (similar to dns-0x20 in its terribleness but 
also
> in the ability to deploy it without a forklift of the whole 
infrastructure),
> which would make it little bit harder to spoof .COM delegation 
responses.

Agree

Roy


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From owner-namedroppers@ops.ietf.org  Thu Aug  7 10:34:11 2008
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On Thu, 7 Aug 2008, Paul Vixie wrote:
>
> first, we should not send, or if we receive, we should not cache or forward,
> anything in the additional section that could be found using a new query.
> this rules out all records except those referred to by NS RRs in an authority
> or answer section, whose target names are at-or-below the NS RR owner name.
>
> second, use these "glue" records only when trying to reach these nameservers,
> or when answering questions or sending referrals about these nameservers.  do
> not use them in answer sections, nor as additional data for MX or SRV or any
> other purpose.  if needed for such "other purpose", go fetch them normally.

Also, these glue records (both authority and additional) should be ignored
if they are already in the cache.

Tony.
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From owner-namedroppers@ops.ietf.org  Thu Aug  7 10:42:01 2008
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From: bert hubert <bert.hubert@netherlabs.nl>
To: Paul Vixie <vixie@isc.org>
Cc: Brian Dickson <briand@ca.afilias.info>,
	Wouter Wijngaards <wouter@NLnetLabs.nl>,
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Subject: Re: Forgery resilience idea - wildcard cooperative defense
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On Thu, Aug 07, 2008 at 05:18:28PM +0000, Paul Vixie wrote:
> any solution requiring cooperative action/change by both the RDNS and ADNS
> has a cost that's equivilent to "deploy DNSSEC".  the thing that's good

That's simply not true - DNSSEC does not function automatically even if both
ADNS and RDNS support it. 

DNSSEC needs a change to:
	ADNS,
	RDNS, 
	the zone, 
	the registry, 
	the registrar,
	and even the operational procedures of domain owner.
	(the stub, the application - if you want to give the end-user a
	choice)

EDNS PING or other entropy enhancing solutions provide benefit to anybody
deploying them, without further work, and require only ADNS and RDNS work.

DNSSEC provides lots of other things beyond entropy of course. 

	Bert

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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Date: Thu, 07 Aug 2008 13:49:47 -0400
From: Brian Dickson <briand@ca.afilias.info>
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To: bert hubert <bert.hubert@netherlabs.nl>, Paul Vixie <vixie@isc.org>, 
 Wouter Wijngaards <wouter@NLnetLabs.nl>,
 Namedroppers <namedroppers@ops.ietf.org>, 
 dns-operations@lists.oarci.net
Subject: Re: Forgery resilience idea - wildcard cooperative defense
References: <489AD5E3.20708@nlnetlabs.nl> <45759.1218122552@nsa.vix.com> <489B295C.3020002@ca.afilias.info> <59360.1218129508@nsa.vix.com> <20080807173819.GA25195@outpost.ds9a.nl>
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bert hubert wrote:
> On Thu, Aug 07, 2008 at 05:18:28PM +0000, Paul Vixie wrote:
>   
>> any solution requiring cooperative action/change by both the RDNS and ADNS
>> has a cost that's equivilent to "deploy DNSSEC".  the thing that's good
>>     
>
> That's simply not true - DNSSEC does not function automatically even if both
> ADNS and RDNS support it. 
>
> DNSSEC needs a change to:
> 	ADNS,
> 	RDNS, 
> 	the zone, 
> 	the registry, 
> 	the registrar,
> 	and even the operational procedures of domain owner.
> 	(the stub, the application - if you want to give the end-user a
> 	choice)
>
>   

Paul's point was that there are orders (many) of magnitude more systems 
enumerated in the sets { ADNS } and { RDNS } than in all the rest of the 
items.

And, if you are talking about touching them, you may as well touch them 
in a way that facilitates DNSSEC - possibly in addition to other things.

Furthermore:
"the zone" and "the registry" are often under the same administrative 
control, and in the case of TLDs, (a) there are very few currently, and 
(b) there are choices of TLD once there exists one TLD that does DNSSEC.

And, technically, it only requires a change to ONE registrar, to enable 
DNSSEC, since it is possible to change registrars, if one wants DNSSEC.

So, the bare minimum for DNSSEC deployment is:
ADNS, RDNS, *one* zone + registry, *one* registrar, and the ops 
procedures and tools for the domain owner - which may be further 
facilitated by the outsourcing of some aspects of domain maintenance to 
a DNS hosting provider that "does" DNSSEC.

Brian

> EDNS PING or other entropy enhancing solutions provide benefit to anybody
> deploying them, without further work, and require only ADNS and RDNS work.
>
> DNSSEC provides lots of other things beyond entropy of course. 
>
> 	Bert
>
>   


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From owner-namedroppers@ops.ietf.org  Thu Aug  7 11:21:06 2008
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Date: Thu, 7 Aug 2008 13:44:34 -0400
To:  Namedroppers <namedroppers@ops.ietf.org>
From: Edward Lewis <Ed.Lewis@neustar.biz>
Subject: Re: Additional filtering of responses
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At 18:32 +0200 8/7/08, Roy Arends wrote:

>What does the scripture say about the following, very small (see * below)
>response:
>
>;; ->>HEADER<<- opcode: QUERY, status: NOERROR, id: 37612
>;; flags: qr aa; QUERY: 1, ANSWER: 1, AUTHORITY: 1, ADDITIONAL: 0
>
>;; QUESTION SECTION:
>;010a.example.          IN      A
>
>;; ANSWER SECTION:
>010a.example.           86400   IN      A       192.0.2.9
>
>;; AUTHORITY SECTION:
>example.                86400   IN      NS      010a.example.
>
>;; Query time: 3 msec
>;; SERVER: 192.0.2.10#53(192.0.2.10)

What bothers me about this is that the SERVER: address is not in the 
list (of 1) addresses authoritative for the zone owning the QNAME. 
(That is, 192.0.2.10 is not 192.0.2.9.)

I would probably reject this as an inappropriate setting of the AA 
bit - or chalk it up to an old BIND recursive server giving me a copy 
back of what it had just gotten from an authoritative server.

If I were paranoid, reject.  If I were paranoid but trying to be 
flexible, i would try to determine the vintage of what was at 
192.0.2.10 and then decide on rejection.  Otherwise, it seems like a 
valid answer.
-- 
-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-
Edward Lewis                                                +1-571-434-5468
NeuStar

Never confuse activity with progress.  Activity pays more.

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 12:07:05 2008
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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
Date: Thu, 7 Aug 2008 21:02:42 +0200
References: <489AD5E3.20708@nlnetlabs.nl> <20080807134236.GA19024@outpost.ds9a.nl>
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Bert,

Imagine a person that has spend considerable amount of time, money and  
energy in implementing DNSSEC in servers, tools and libraries; has  
'evanginered' DNSSEC for years in a consistently balanced way,  
recognizing that implementing DNSSEC is far from easy; and has  
provided multiple pieces of documentation. In other words a person who  
has put the money where the mouth is.

How would such person defend against being assessed to suffer from  
groupthink or tunnelvission?

Every word such a person would utter in defense would be to responded  
to as "That person has a vetted interest and is part of the  
groupthinking tunnelvisionaires".

These sort of remarks are not very helpful for constructive  
engineering and don't help to get the core of your message across:  
"Keep an open mind in alternative interim(?) approaches and work on  
making DNSSEC easier to operate"


--Olaf




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On Thu, 7 Aug 2008, Edward Lewis wrote:

> What bothers me about this is that the SERVER: address is not in the list (of
> 1) addresses authoritative for the zone owning the QNAME. (That is, 192.0.2.10
> is not 192.0.2.9.)

dig's server is the rDNS, not the aDNS.

Tony.
-- 
f.anthony.n.finch  <dot@dotat.at>  http://dotat.at/
SHANNON ROCKALL: NORTHERLY BACKING SOUTHERLY 5 OR 6, OCCASIONALLY 7 LATER.
MODERATE OR ROUGH. SHOWERS. MAINLY GOOD.

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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
Date: Thu, 7 Aug 2008 13:12:09 -0700
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Bert,

On Aug 7, 2008, at 6:42 AM, bert hubert wrote:
> On Thu, Aug 07, 2008 at 01:00:51PM +0200, Wouter Wijngaards wrote:
>> The best solution is of course DNSSEC. Crypto signatures instead of
>> randomisation games. Enable DNSSEC validation now.
> Not specifically aimed at you Wouter, but it appears the most vocal  
> people
> in the DNS world are starting to suffer from "groupthink".

If constructive discussion is desirable, I suspect it would probably  
be best to avoid labeling.

> The reason I rant on about this is that I care deeply about DNS, and  
> that
> DNS is *currently* under attack. While DNSSEC is agressively branded  
> as a
> fine solution, at best, it will be a solution in a few years.

This isn't quite accurate.  DNSSEC is an incrementally deployable  
solution.  It can fully protect zones that take the trouble to sign  
today if caching server operators take the trouble to configure trust  
anchors for those zones.  I have some skepticism DNSSEC will be a  
fully deployed solution in the foreseeable future, however that does  
not mean that there isn't potential benefit from its use.

And I say this as someone who hates DNSSEC with the passion of a  
thousands suns of passionate hate.

> Additionally, given things I've said before, I personally don't  
> think DNSSEC
> will ever see wide usage in the real world, so I feel very strongly  
> that not
> only do we need to improve DNS in the short term, the short term  
> solution
> also needs to be the long term solution.

The short term solutions proposed to date are protecting the data  
_channel_, not the actual data itself.  Fundamentally, this is a  
flawed approach because as long as the data in the response is  
vulnerable, there will be ways to abuse it.  Perfect source port/128  
bit XQID randomization, query/response TTL windowing, whatever is  
meaningless if you have write access to the path over which the query  
or response travels.  Those hacks are treating the symptom and are a  
holding action whereas DNSSEC, like aggressive chemotherapy, treats  
the disease.  One can reasonably argue that the side effects of  
treating the disease may be worse than the disease, but my view is  
that is simply a "small matter of programming" that will be addressed  
over time.

> But no matter what I feel - please everybody take a minute to read the
> symptoms of groupthink, and wonder if we are still doing the best  
> job we can
> to improve DNS in the real world.

I will admit that this feels sort of like someone from the petroleum  
industry accusing folks at the IPCC of "groupthink".

In the end, rants on either side don't actually matter all that much.   
There is a problem for which DNSSEC is proposed as a solution.  There  
are implementations that both do and do not support DNSSEC.  There are  
costs, benefits, and risks on which individual organizations will have  
to base their decisions to deploy DNSSEC or not. As such, I can't get  
too worked up on this topic -- I suspect the market will decide.

Regards,
-drc


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Date: Thu, 7 Aug 2008 22:47:08 +0200
From: bert hubert <bert.hubert@netherlabs.nl>
To: Olaf Kolkman <olaf@NLnetLabs.nl>
Cc: Namedroppers <namedroppers@ops.ietf.org>
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
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On Thu, Aug 07, 2008 at 09:02:42PM +0200, Olaf Kolkman wrote:
> Imagine a person that has spend considerable amount of time, money and  
> energy in implementing DNSSEC in servers, tools and libraries; has  
> 'evanginered' DNSSEC for years in a consistently balanced way,  
> recognizing that implementing DNSSEC is far from easy; and has  
> provided multiple pieces of documentation. In other words a person who  
> has put the money where the mouth is.

Olaf - I can imagine only too well. Around 7 years ago I attended a talk by
you where you publicly wondered out loud which problem DNSSEC would solve,
and how it could actually be implemented. I was impressed by your
open-mindedness.

Over the years, I've seen the open mindedness disappear from the community.

As a decade passed away and DNSSEC stil hadn't caught on, self-doubt has
been replaced by the mantra that DNSSEC will soon be deployed, and that it
is ready - when there is much still up in the air.

> How would such person defend against being assessed to suffer from  
> groupthink or tunnelvission?

That is very valid criticism, and I spent quite some time tonight figuring
out what I'm actually hoping to achieve - besides what is described very
well on http://xkcd.com/386/ . 

The main thing I hope is that we won't forget the pre-DNSSEC world. In short
this means committing towards finding a solution in short order that will
address remaining spoofing dangers - 64% chance of success within 24 hours
using reasonable resources. Success in these terms might be "effectively
taking over the root for 100000 people".

I've already seen influential WG members state that we'll have only one
chance to seriously change DNS in the coming decade. And furthermore, that
we should use this one chance for implementing DNSSEC.

In addition, it has been reasoned that implementing DNSSEC is just as hard
or easy as implementing entropy additions.

The upshot of this all is that people are effectively saying they will not
be supporting anything *but* DNSSEC.

And that would be sad, if not dangerous, especially since quite a number of
wise people agree DNSSEC rollout will take years. We don't have years to
address the 64% chance.

> These sort of remarks are not very helpful for constructive  
> engineering and don't help to get the core of your message across:  
> "Keep an open mind in alternative interim(?) approaches and work on  
> making DNSSEC easier to operate"

I'd love to be able to put it less bluntly. What is also not helpful is the
near-religious mantra that DNSSEC is the only solution, a mantra which is
part of an astoundingly large part of recent postings and literature.

So - I apologise for accusing people of something it is hard to defend
against. 

But I sincerely hope we won't let the dream of large-scale DNSSEC deployment
over time stand in the way of doing something now.

	Bert

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 14:03:11 2008
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References: <489AD5E3.20708@nlnetlabs.nl> <45759.1218122552@nsa.vix.com>
 <OF8C6AC1F0.001ADC24-ON8025749E.00576A89-C125749E.005ADCE2@nominet.org.uk>
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Date: Thu, 7 Aug 2008 16:44:05 -0400
To: Tony Finch <dot@dotat.at>
From: Edward Lewis <Ed.Lewis@neustar.biz>
Subject: Re: Additional filtering of responses
Cc: Edward Lewis <Ed.Lewis@neustar.biz>,
        Namedroppers <namedroppers@ops.ietf.org>
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At 20:03 +0100 8/7/08, Tony Finch wrote:
>On Thu, 7 Aug 2008, Edward Lewis wrote:
>
>>  What bothers me about this is that the SERVER: address is not in 
>>the list (of
>>  1) addresses authoritative for the zone owning the QNAME. (That 
>>is, 192.0.2.10
>>  is not 192.0.2.9.)
>
>dig's server is the rDNS, not the aDNS.

Ok, but still, the aa bit would then make me do some more sanity 
checking if I were paranoid.

Is(n't) it true that BIND 9 no longer sets AA bit on answers a'coming 
through the cache?
-- 
-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-
Edward Lewis                                                +1-571-434-5468
NeuStar

Never confuse activity with progress.  Activity pays more.

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 14:07:42 2008
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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
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I have read Hubert-DNSSEC-groupthink and support its adoption as a WG 
document :-)

  -F

bert hubert wrote:
> On Thu, Aug 07, 2008 at 01:00:51PM +0200, Wouter Wijngaards wrote:
>> The best solution is of course DNSSEC. Crypto signatures instead of
>> randomisation games. Enable DNSSEC validation now.
> 
> Not specifically aimed at you Wouter, but it appears the most vocal people
> in the DNS world are starting to suffer from "groupthink". 
> 
> http://en.wikipedia.org/wiki/Groupthink
> 
> "A mode of thinking that people engage in when they are deeply involved in a
>  cohesive in-group, when the members' strivings for unanimity override their
>  motivation to realistically appraise alternative courses of action"
> 
> "Groupthink tends to occur on committees and in large organizations. 
>  [..]"
> 
> For a fine compendium of the kind of statements I mean, please see
> http://www.dnssec-deployment.org/news/dnssecthismonth/current/
> 
> 	DNSSEC cited as "only full solution" to recent DNS vulnerability
> 
> 	"DNSSEC is the only full solution."
> 
> 	"We at ISC hope that this issue will draw attention to DNSSEC, which
> 	in the end will only be the real solution"
> 
> And this can't be good - it is leading us to make statements which are
> patently untrue, like "turn on DNSSEC to be safe".
> 
> Or 79 page presentations called "DNSSEC in six minutes" - giving people 4.6
> seconds per page. It is just not real.
> http://www.isc.org/sw/bind/docs/DNSSEC_in_6_minutes.pdf 
> 
> Or asking people repeatedly to remove the phrase "under development" when
> DNSSEC is referred to as a solution under development - which it patently
> is. 
> 
> If the goal is to deploy DNSSEC quickly, roll out the tools surrounding it,
> invent the protocols for getting your keying material upstream, widen the
> registry-registrar protocols to fit these records, create the emergency key
> rollover procedures (and don't hide the need for them), implement 'auto-sign
> yes;' etc etc etc. The only way DNSSEC will ever work if it is only slightly
> harder to operate than DNS.
> 
> But if you care about DNSSEC, please stop pretending DNSSEC is ready to
> deploy and just waiting for people to get around to it.
> 
> If you care about DNSSEC, don't hide that it might in itself have security
> implications.
> 
> If you care about DNSSEC, please also stop pretending it is not far harder
> to operate than DNS itself. DNS is already considered to be difficult, and
> operators mess it up all the time. It is not like adding an 's' to
> 'http://'.
> 
> All these things will come back to haunt you when people actually do follow
> the advice to turn on DNSSEC now, and discover they've either done something
> that doesn't help (signing without getting the trust anchor used), or have
> actually caused their domains to go down, because they did not
> institutionalize the key rollover procedures.
> 
> ("You mean this goes down if I don't re-sign in time? Wow!").
> 
> The reason I rant on about this is that I care deeply about DNS, and that
> DNS is *currently* under attack. While DNSSEC is agressively branded as a
> fine solution, at best, it will be a solution in a few years.
> 
> Additionally, given things I've said before, I personally don't think DNSSEC
> will ever see wide usage in the real world, so I feel very strongly that not
> only do we need to improve DNS in the short term, the short term solution
> also needs to be the long term solution.
> 
> But no matter what I feel - please everybody take a minute to read the
> symptoms of groupthink, and wonder if we are still doing the best job we can
> to improve DNS in the real world. 
> 
> Because that is our goal. I hope. 
> 
> 	Bert
> 


-- 

_________________________________________
-- "'Problem' is a bleak word for challenge" - Richard Fish
(Federico L. Lucifredi) - flucifredi@ximian.com


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In-Reply-To: Your message of "Thu, 07 Aug 2008 16:44:05 -0400."
             <a06240800c4c10e41c8a1@[10.31.201.66]> 
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> Is(n't) it true that BIND 9 no longer sets AA bit on answers a'coming
> through the cache?

yes.  everything is cached and regenerated.  bind9 RDNS never sets AA.

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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
References: <489AD5E3.20708@nlnetlabs.nl> <20080807134236.GA19024@outpost.ds9a.nl>  <489B09FE.8050701@e164.org> <49451.1218124457@nsa.vix.com>
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Paul Vixie wrote:
> you are both missing the point of that document.  it's not a six minute
> presentation.  but after you sit through that presentation, you can get
> dnssec running in six minutes.  (we've measured.)  which is not to say
> that dnssec is easy -- i know that at ISC we're thinking seriously of
> dedicating the whole BIND 9.7 release to dnssec tools and usability.

I never mentioned anything about the time of the presentation or time to
set it up, my comment was how convoluted and complicated the process is
caused me to to instantly dislike it due to that reason.

> you can use whatever TTL you want.  but more importantly, are you saying

I realise this, but I was under the mistaken assumption, before Bert
corrected me that sigs were generated on the fly and were only valid for
a small window.

> we should discard a protocol because of the quality of early implementations
> especially in terms of usability?  because if that were true i'm pretty
> sure TCP/IP should have been shot dead back in 1985 or so.  likewise X11,
> BSD, Linux, Windows, and MAC/OS.

Ummm a good 'security' model in this sense would be to look at the
credit card industry, unless payment gateways are down merchants are
instantly notified of problems with credit cards, not 30 days later.

> duane, i understand why bert's a dnssec denier.  but i urge you to study
> the historical debates and the threat models document and think carefully
> before you climb on that bandwagon.

Oh please give me a little credit here and drop the 'denier' nonsense
right now, that term is often used as an emotive response that has no
basis in logic or reason where the underlying argument is weak in order
to silence criticisms.

-- 

Best regards,
 Duane

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Cc: bert hubert <bert.hubert@netherlabs.nl>,
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS 
In-reply-to: Your message of "Fri, 08 Aug 2008 00:43:10 +1000."
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> bert hubert wrote:
> > Or 79 page presentations called "DNSSEC in six minutes" - giving people 4.6
> > seconds per page. It is just not real.
> > http://www.isc.org/sw/bind/docs/DNSSEC_in_6_minutes.pdf 
> 
> I've seen this document in the past and it actually turned me and others
> completely off the idea of DNSSEC, which in part was what led to me
> playing with encryption funnily enough, because it seems to me most are
> promoting 30 day TTLs on the sigs, which means 30 days of replay attacks
> potentially,

	and the alterative is arbitary data insertion.

	You could have online keys and sign every response with a
	ttl + clock skew based window.  This requires that the
	private key is on all slaves.  The crypto hardware guys
	will love you :-)

	Note this is a implementation / deployment trade off.  The
	protocol supports either senario.

> not to mention the whole re-signing every 30 days.

	Which can be completely automated.  Has already been in
	some senarios.  I havn't re-signed my zones for months
	despite using a 30 day expiry period on the signatures.

	It is set and forget.  More and more of the process will
	become "set and forget" as the tools develop.

> Who ever thought that does not live in the real world, people
> administering servers with X.509 certs that expire yearly is bad enough,
> but every 30 days or less???

	Well if you know that the data will be stable for a year
	you can sign once a year.
 
> That alone is going to be a show stopped for most if not all admins with
> too many things to do and not enough time to do everything.

	The tools today can take a signed zone and re-sign it as
	well as incrementing the SOA serial in the process.  Re-signing
	then reloading can be run from cron on a weekly basis.

	Note the tools will only get better so the costs will
	continue to go down.  They have gone down enormously from
	the original design costs.

	Mark
> -- 
> 
> Best regards,
>  Duane
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
References: <489AD5E3.20708@nlnetlabs.nl> <20080807134236.GA19024@outpost.ds9a.nl> <F153E1C5-6E05-475A-897D-471398D161C9@NLnetLabs.nl>
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Olaf Kolkman wrote:

> Imagine a person that has spend considerable amount of time, money and
> energy in implementing DNSSEC in servers, tools and libraries; has
> 'evanginered' DNSSEC for years in a consistently balanced way,
> recognizing that implementing DNSSEC is far from easy; and has provided
> multiple pieces of documentation. In other words a person who has put
> the money where the mouth is.

You summed it up so nicely, they have put so much time and effort into
this that they can't see if there are other options because they are
blinded by the blinkers they have on, to go forward no matter what the
cost or no matter what other solutions could solve the same problem.

> How would such person defend against being assessed to suffer from
> groupthink or tunnelvission?

All I've heard lately is shouts of enable DNSSEC now, or die, frankly
I'm not very moved by them nor anyone else I know, it's 2008 and DNSSEC
is using a model even X.509 threw out years ago and has been trying to
fix every since.

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 18:14:45 2008
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Mark Andrews wrote:
> 	and the alterative is arbitary data insertion.
> 
> 	You could have online keys and sign every response with a
> 	ttl + clock skew based window.  This requires that the
> 	private key is on all slaves.  The crypto hardware guys
> 	will love you :-)

I'm working on it, I'm fighting 2 issues at present, one to standardise
attributes on OpenPGP keys for server purposes, and once that's sorted
and all the hubbub about DNS has died down the 2nd issue is using
encryption to provide both confidentiality and effectively remove the
need for signing at all.

Thanks to feed back from people in this group I've improve the draft
considerably but yea, the idea now is to setup a AES session key that is
good for X hours using an initial RSA encrypted request from the client.

> 	Note this is a implementation / deployment trade off.  The
> 	protocol supports either senario.

It's 2008 and hardware is cheap it's silly to think of 1960's credit
card processing models are even valid 10 years ago let alone now.

> 	Which can be completely automated.  Has already been in
> 	some senarios.  I havn't re-signed my zones for months
> 	despite using a 30 day expiry period on the signatures.

Shows how much DNSSEC is used by you then, otherwise you would be
rejecting your own DNS replies.

> 	It is set and forget.  More and more of the process will
> 	become "set and forget" as the tools develop.

You miss the point, that presentation outlined what is now, not what
will be when someone can be bothered to.

> 	Well if you know that the data will be stable for a year
> 	you can sign once a year.

At the vest least natural disasters don't stick to time tables last time
I checked.

> 	The tools today can take a signed zone and re-sign it as
> 	well as incrementing the SOA serial in the process.  Re-signing
> 	then reloading can be run from cron on a weekly basis.

That's a nice 'hack'

> 	Note the tools will only get better so the costs will
> 	continue to go down.  They have gone down enormously from
> 	the original design costs.

Again, I can only comment on what is, not what will be.

-- 

Best regards,
 Duane

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duane, if your point is that dnssec is horrid misshapen pig that even
its mother could not love, then you will find noone (anywhere) willing
to argue otherwise.  it's late, it's ugly, it's fragile, it's a pig,
and that's the universal view of it, there are no dissenters.

but having ridden the whole ride and having seen victory declared several
times, i am in the "it can be made to work in its present form without any
more flag days" camp.  call that groupthink if you must, say what you want
about me, but say also that i hate dnssec but plan to deploy it anyway.

--paul

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> From: Duane <duane@e164.org>
> 
> You summed it up so nicely, they have put so much time and effort into
> this that they can't see if there are other options because they are
> blinded by the blinkers they have on, to go forward no matter what the
> cost or no matter what other solutions could solve the same problem.

as a possible proposed "they" in that example, i wonder what other option
will allow arbitrary end users to be sure that an NXDOMAIN has not been
remapped by their ISP or by their RDNS?  or that a secondary name service
provider (or a primary name service provider for that matter) hasn't added
a wildcard to catch typo's in their customer domains and send them to an
advertising server?  in other words, what other options provide end-to-end
data integrity for DNS?  if all you've got is hop-by-hop, i'm uninterested.

amit klein and dan kaminsky have showed us some off-path attacks, to which
dan bernstein and amit klein and david dagon have shown us some RDNS-only
defenses.  but provider-in-the-middle and more generally man-in-the-middle
attacks are on-path not off-path.  i want protection against on-path
attacks, as well as against all possible future off-path attacks.  you're
right that i'm dismissing proposals that do not address those requirements.
now you know exactly why.

> > How would such person defend against being assessed to suffer from
> > groupthink or tunnelvission?
> 
> All I've heard lately is shouts of enable DNSSEC now, or die, frankly
> I'm not very moved by them nor anyone else I know, it's 2008 and DNSSEC
> is using a model even X.509 threw out years ago and has been trying to
> fix every since.

after watching masataka's superior approach get railroaded into a ditch
back in 1996 or 1997 or so, i can no longer get bogged down in how ugly
the protocol is or how ugly was the process that begat that protocol.  my
pragmatic concerns are only, is it end-to-end, and can it be made to work?

show me an option that's end-to-end and can be made to work and i'll pay
close attention and if it's real i'll say "dnssec or this other thing are
the only real solutions."

but show me a hop-by-hop solution and i'll say "this isn't complete" and if
it requires a replacement or upgrade of both RDNS and ADNS nodes then i'll
say "at that price i'd prefer end-to-end data integrity, please."

let's stop talking personalities and focus on the engineering economics.

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To: Duane <duane@e164.org>
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        Namedroppers <namedroppers@ops.ietf.org>
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS 
In-reply-to: Your message of "Fri, 08 Aug 2008 11:10:19 +1000."
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> Mark Andrews wrote:
> > 	and the alterative is arbitary data insertion.
> > 
> > 	You could have online keys and sign every response with a
> > 	ttl + clock skew based window.  This requires that the
> > 	private key is on all slaves.  The crypto hardware guys
> > 	will love you :-)
> 
> I'm working on it, I'm fighting 2 issues at present, one to standardise
> attributes on OpenPGP keys for server purposes, and once that's sorted
> and all the hubbub about DNS has died down the 2nd issue is using
> encryption to provide both confidentiality and effectively remove the
> need for signing at all.
> 
> Thanks to feed back from people in this group I've improve the draft
> considerably but yea, the idea now is to setup a AES session key that is
> good for X hours using an initial RSA encrypted request from the client.
> 
> > 	Note this is a implementation / deployment trade off.  The
> > 	protocol supports either senario.
> 
> It's 2008 and hardware is cheap it's silly to think of 1960's credit
> card processing models are even valid 10 years ago let alone now.
> 
> > 	Which can be completely automated.  Has already been in
> > 	some senarios.  I havn't re-signed my zones for months
> > 	despite using a 30 day expiry period on the signatures.
> 
> Shows how much DNSSEC is used by you then, otherwise you would be
> rejecting your own DNS replies.

	I missed the "by hand" part.

	I havn't re-signed my zones, by hand, for months despite
	using a 30 day expiry period on the signatures. 

	Completely automated re-signing.
 
> > 	It is set and forget.  More and more of the process will
> > 	become "set and forget" as the tools develop.
> 
> You miss the point, that presentation outlined what is now, not what
> will be when someone can be bothered to.
> 
> > 	Well if you know that the data will be stable for a year
> > 	you can sign once a year.
> 
> At the vest least natural disasters don't stick to time tables last time
> I checked.
> 
> > 	The tools today can take a signed zone and re-sign it as
> > 	well as incrementing the SOA serial in the process.  Re-signing
> > 	then reloading can be run from cron on a weekly basis.
> 
> That's a nice 'hack'
> 
> > 	Note the tools will only get better so the costs will
> > 	continue to go down.  They have gone down enormously from
> > 	the original design costs.
> 
> Again, I can only comment on what is, not what will be.
> 
> -- 
> 
> Best regards,
>  Duane
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 19:22:57 2008
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To: Edward Lewis <Ed.Lewis@neustar.biz>
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: Additional filtering of responses 
In-reply-to: Your message of "Thu, 07 Aug 2008 16:44:05 -0400."
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> At 20:03 +0100 8/7/08, Tony Finch wrote:
> >On Thu, 7 Aug 2008, Edward Lewis wrote:
> >
> >>  What bothers me about this is that the SERVER: address is not in 
> >>the list (of
> >>  1) addresses authoritative for the zone owning the QNAME. (That 
> >>is, 192.0.2.10
> >>  is not 192.0.2.9.)
> >
> >dig's server is the rDNS, not the aDNS.
> 
> Ok, but still, the aa bit would then make me do some more sanity 
> checking if I were paranoid.
> 
> Is(n't) it true that BIND 9 no longer sets AA bit on answers a'coming 
> through the cache?

	It *never* set AA on answers from the cache.  All remote answers
	go through the cache.

	AA is only set on answers from zone data.

> -- 
> -=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-
> Edward Lewis                                                +1-571-434-5468
> NeuStar
> 
> Never confuse activity with progress.  Activity pays more.
> 
> --
> to unsubscribe send a message to namedroppers-request@ops.ietf.org with
> the word 'unsubscribe' in a single line as the message text body.
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-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS 
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> Ummm a good 'security' model in this sense would be to look at the
> credit card industry, unless payment gateways are down merchants are
> instantly notified of problems with credit cards, not 30 days later.

	Well we could stop caching any DNS data.  That's the only
	way to make it match the credit card industry model where
	changes are instantly available.

	Mark
-- 
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PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 19:59:12 2008
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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
References: <489AD5E3.20708@nlnetlabs.nl> <20080807134236.GA19024@outpost.ds9a.nl> <489B09FE.8050701@e164.org> <49451.1218124457@nsa.vix.com>  <489B98FA.40307@e164.org> <26046.1218159498@nsa.vix.com>
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Paul Vixie wrote:
> duane, if your point is that dnssec is horrid misshapen pig that even
> its mother could not love, then you will find noone (anywhere) willing
> to argue otherwise.  it's late, it's ugly, it's fragile, it's a pig,
> and that's the universal view of it, there are no dissenters.

No arguments here.

> but having ridden the whole ride and having seen victory declared several
> times, i am in the "it can be made to work in its present form without any
> more flag days" camp.  call that groupthink if you must, say what you want
> about me, but say also that i hate dnssec but plan to deploy it anyway.

I most sincerely apologise if I made any person comment to or about you
that most certainly was not my intention. I like everyone else want a
solution to this and other problems with DNS but for a number of reasons
I don't like the form it's taken in DNSSEC.

I'm trying to stick to the non-political factual reasons for my concerns
over it, however it wouldn't be terribly difficult to figure out other
concerns I have with it.

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 20:13:38 2008
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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
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Paul Vixie wrote:

> as a possible proposed "they" in that example, i wonder what other option
> will allow arbitrary end users to be sure that an NXDOMAIN has not been
> remapped by their ISP or by their RDNS?  or that a secondary name service
> provider (or a primary name service provider for that matter) hasn't added
> a wildcard to catch typo's in their customer domains and send them to an
> advertising server?  in other words, what other options provide end-to-end
> data integrity for DNS?  if all you've got is hop-by-hop, i'm uninterested.

I maybe late to this party but I tried to engage you in this in previous
email correspondences, suffice to say I don't think either of us have
all the answers but dismissing alternative opinions on how this could be
solved out of hand isn't going to help either.

> amit klein and dan kaminsky have showed us some off-path attacks, to which
> dan bernstein and amit klein and david dagon have shown us some RDNS-only
> defenses.  but provider-in-the-middle and more generally man-in-the-middle
> attacks are on-path not off-path.  i want protection against on-path
> attacks, as well as against all possible future off-path attacks.  you're
> right that i'm dismissing proposals that do not address those requirements.
> now you know exactly why.

You just pointed out the solution, and I'm pretty sure you or others
have mentioned this before, but as far as end to end solutions go the
only solution is to run the resolving DNS caching at the end points.

While this negates some of the benefits of caching by say ISPs, it's
more than obvious the ISPs can no longer be trusted on that front in any
case and end user directly requesting to authoritative DNS servers is
the only option.

After all, do we allow ISPs to cache SSL connections, why should DNS be
any different?

> after watching masataka's superior approach get railroaded into a ditch
> back in 1996 or 1997 or so, i can no longer get bogged down in how ugly
> the protocol is or how ugly was the process that begat that protocol.  my
> pragmatic concerns are only, is it end-to-end, and can it be made to work?

How much enthusiasm has been garnered for DNSSEC since well ever except
by those evangelising it?

If you can't sell it to people like me purely on its merits it's already
a forgone conclusion, I'm not trying to be facetious here or
antagonistic but pointing out a reality of the way the world is, not the
way we'd like the world to be.

> but show me a hop-by-hop solution and i'll say "this isn't complete" and if
> it requires a replacement or upgrade of both RDNS and ADNS nodes then i'll
> say "at that price i'd prefer end-to-end data integrity, please."

You've already outlined numerous corner cases where DNSSEC will fail in
end to end data integrity, so obviously it's not solving the issue in
all cases either.

My hop-by-hop approach wasn't the end game, merely a stepping stone
until something better could occur at the end points, my approach is
simply trying to go the path of least resistance and work up from there.

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 20:18:28 2008
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Mark Andrews wrote:

> 	Well we could stop caching any DNS data.  That's the only
> 	way to make it match the credit card industry model where
> 	changes are instantly available.

Anyone have any idea how many credit card transactions per second occur?

Seems to me they are very similar in topology, so even if you only
cached information for a small amount of time that would mitigate most
attacks people seem to be so concerned about at present.

Since the window of opportunity for these sort of attacks would be
greatly reduced, the cost to commit these types of attacks would greatly
increase if not be virtually impossible to commit on any kind of scale
worth doing, so problem solved.

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 20:38:42 2008
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS 
In-reply-to: Your message of "Fri, 08 Aug 2008 13:14:36 +1000."
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> Mark Andrews wrote:
> 
> > 	Well we could stop caching any DNS data.  That's the only
> > 	way to make it match the credit card industry model where
> > 	changes are instantly available.
> 
> Anyone have any idea how many credit card transactions per second occur?
> 
> Seems to me they are very similar in topology, so even if you only
> cached information for a small amount of time that would mitigate most
> attacks people seem to be so concerned about at present.
> 
> Since the window of opportunity for these sort of attacks would be
> greatly reduced, the cost to commit these types of attacks would greatly
> increase if not be virtually impossible to commit on any kind of scale
> worth doing, so problem solved.

	Except it wouldn't solve NXDOMAIN re-writing and other
	on-path attacks which modify the returned data such that
	it is believed.

	Mark

-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 20:45:47 2008
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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
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Mark Andrews wrote:

> 	Except it wouldn't solve NXDOMAIN re-writing and other
> 	on-path attacks which modify the returned data such that
> 	it is believed.

Others have pointed out other cases where DNSSEC won't either. Reducing
the caching time only requires changes at the resolver end, unlike
DNSSEC which if Bert's list is accurate is quite long and involved code
wise.

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 20:48:41 2008
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS 
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> Paul Vixie wrote:
> 
> > as a possible proposed "they" in that example, i wonder what other option
> > will allow arbitrary end users to be sure that an NXDOMAIN has not been
> > remapped by their ISP or by their RDNS?  or that a secondary name service
> > provider (or a primary name service provider for that matter) hasn't added
> > a wildcard to catch typo's in their customer domains and send them to an
> > advertising server?  in other words, what other options provide end-to-end
> > data integrity for DNS?  if all you've got is hop-by-hop, i'm uninterested.
> 
> I maybe late to this party but I tried to engage you in this in previous
> email correspondences, suffice to say I don't think either of us have
> all the answers but dismissing alternative opinions on how this could be
> solved out of hand isn't going to help either.
> 
> > amit klein and dan kaminsky have showed us some off-path attacks, to which
> > dan bernstein and amit klein and david dagon have shown us some RDNS-only
> > defenses.  but provider-in-the-middle and more generally man-in-the-middle
> > attacks are on-path not off-path.  i want protection against on-path
> > attacks, as well as against all possible future off-path attacks.  you're
> > right that i'm dismissing proposals that do not address those requirements.
> > now you know exactly why.
> 
> You just pointed out the solution, and I'm pretty sure you or others
> have mentioned this before, but as far as end to end solutions go the
> only solution is to run the resolving DNS caching at the end points.

I don't think anyone would disagree with you.  Preferably validation
should be done in the application.  If that is not supported by the
application then on the local machine.

Validation in off machine caches is only there for the legacy machines.

> While this negates some of the benefits of caching by say ISPs, it's
> more than obvious the ISPs can no longer be trusted on that front in any
> case and end user directly requesting to authoritative DNS servers is
> the only option.

Only if the ISP's don't supply clean path.  DNSSEC allows you to
detect when the path has been compromised.

> After all, do we allow ISPs to cache SSL connections, why should DNS be
> any different?
> 
> > after watching masataka's superior approach get railroaded into a ditch
> > back in 1996 or 1997 or so, i can no longer get bogged down in how ugly
> > the protocol is or how ugly was the process that begat that protocol.  my
> > pragmatic concerns are only, is it end-to-end, and can it be made to work?
> 
> How much enthusiasm has been garnered for DNSSEC since well ever except
> by those evangelising it?
> 
> If you can't sell it to people like me purely on its merits it's already
> a forgone conclusion, I'm not trying to be facetious here or
> antagonistic but pointing out a reality of the way the world is, not the
> way we'd like the world to be.
> 
> > but show me a hop-by-hop solution and i'll say "this isn't complete" and if
> > it requires a replacement or upgrade of both RDNS and ADNS nodes then i'll
> > say "at that price i'd prefer end-to-end data integrity, please."
> 
> You've already outlined numerous corner cases where DNSSEC will fail in
> end to end data integrity, so obviously it's not solving the issue in
> all cases either.
> 
> My hop-by-hop approach wasn't the end game, merely a stepping stone
> until something better could occur at the end points, my approach is
> simply trying to go the path of least resistance and work up from there.
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 20:52:48 2008
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Mark Andrews wrote:

> Validation in off machine caches is only there for the legacy machines.

That's always going to be an issue unless you can get all parties to
implement something better.

> Only if the ISP's don't supply clean path.  DNSSEC allows you to
> detect when the path has been compromised.

Only if you already know DNSSEC mechanisms exist and they haven't been
filtered.

-- 

Best regards,
 Duane

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To: Duane <duane@e164.org>
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS 
In-reply-to: Your message of "Fri, 08 Aug 2008 13:45:30 +1000."
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> Mark Andrews wrote:
> 
> > Validation in off machine caches is only there for the legacy machines.
> 
> That's always going to be an issue unless you can get all parties to
> implement something better.

Well every PC owner can do this today.  It is not that hard to setup
a on machine validating caching server and to configure the PC to use
it.

It's only administative inertia that stops people doing it today.

Mark
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 21:23:35 2008
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To: Mark Andrews <Mark_Andrews@isc.org>
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 bert hubert <bert.hubert@netherlabs.nl>,
 Namedroppers <namedroppers@ops.ietf.org>
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
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Mark Andrews wrote:
>> Mark Andrews wrote:
>>
>>> Validation in off machine caches is only there for the legacy machines.
>> That's always going to be an issue unless you can get all parties to
>> implement something better.
> 
> Well every PC owner can do this today.  It is not that hard to setup
> a on machine validating caching server and to configure the PC to use
> it.

Ok so you're saying these people that get suckered by internet/email
scams would be capable of setting this up properly?

> It's only administative inertia that stops people doing it today.

No, there is a lot more to it than that, most people don't understand
internet security, you know it's bad when most people get warm fuzzy
feelings over actions taken to make them feel secure, when the reality
is so far from the truth it's not funny.

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 21:49:12 2008
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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
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Duane wrote:
> Mark Andrews wrote:
>
>   
>> 	Except it wouldn't solve NXDOMAIN re-writing and other
>> 	on-path attacks which modify the returned data such that
>> 	it is believed.
>>     
>
> Others have pointed out other cases where DNSSEC won't either. Reducing
> the caching time only requires changes at the resolver end, unlike
> DNSSEC which if Bert's list is accurate is quite long and involved code
> wise.
>
>   

I don't recall any specific cases being pointed out.

If you wouldn't mind, could you give some kind of reference (e.g. who, 
or what case, or ideally, a URL pointing into the archives)?

To clarify - what DNSSEC does (or at least claims to do) is make it 
possible to validate answers to queries, against a chain of trust to 
some trust anchor.

This means one of three results occurs - a valid answer is confirmed, an 
unverified answer exists due to lack of signature (where the lack of 
signature itself is able to be validated), or tampering occurs and is 
detected.

So, it won't *prevent* tampering, but does make the data itself 
tamper-evident.

Tampering is only slightly worse than a blind DoS attack, and has the 
same results in a DNSSEC-protected world. The only incremental benefit 
of hop-by-hop crypto security would be to  make the data opaque, which 
while in theory seems better, in practice is irrelevant. If you can't 
tamper with the data, it doesn't matter whether you can see it. And 
hop-by-hop data encryption is a bigger cost than validation via 
signatures, particularly in the increase in state, and in the asymmetric 
cost model. Signatures scale very well, especially in an one-to-many 
world, which DNS is.

>> > Only if the ISP's don't supply clean path.  DNSSEC allows you to
>> > detect when the path has been compromised.
>>     
>
> Only if you already know DNSSEC mechanisms exist and they haven't been
> filtered.
>   

??

You can't filter DNSSEC mechanisms without that filtration being 
detected (on a validating resolver).

This includes the ability to determine whether DNSSEC mechanisms exist.

(The above is predicated on some configured trust anchor, either a 
signed root or via locally configured trust anchors, or DLV.)

If you believe these aren't correct statements, I encourage you to 
provide something more than a mere assertion, e.g. example, reference, 
proof, counter-example, or anything else that you think will support 
your position.

BTW - critical analysis of DNSSEC and alternatives is by no means 
discouraged, and I think any time anyone brings fresh eyes to the 
problem, only good things can come of it - if polite, reasoned discourse 
is the result.

Brian

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 21:58:34 2008
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To: Duane <duane@e164.org>
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        bert hubert <bert.hubert@netherlabs.nl>,
        Namedroppers <namedroppers@ops.ietf.org>
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS 
In-reply-to: Your message of "Fri, 08 Aug 2008 14:17:54 +1000."
             <489BC8F2.3040204@e164.org> 
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> Mark Andrews wrote:
> >> Mark Andrews wrote:
> >>
> >>> Validation in off machine caches is only there for the legacy machines.
> >> That's always going to be an issue unless you can get all parties to
> >> implement something better.
> > 
> > Well every PC owner can do this today.  It is not that hard to setup
> > a on machine validating caching server and to configure the PC to use
> > it.
> 
> Ok so you're saying these people that get suckered by internet/email
> scams would be capable of setting this up properly?

People setup caching servers everyday today.  Setting up one to
also do validation is not that much extra.  

> > It's only administative inertia that stops people doing it today.
> 
> No, there is a lot more to it than that, most people don't understand
> internet security, you know it's bad when most people get warm fuzzy
> feelings over actions taken to make them feel secure, when the reality
> is so far from the truth it's not funny.

And education is the solution to that.
 
People aren't as stupid as we often portray then as.  Give them
good information and they will use it.  Do best practice from the
start.

Mark
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 22:17:39 2008
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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
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Brian Dickson wrote:

> I don't recall any specific cases being pointed out.

http://ops.ietf.org/lists/namedroppers/namedroppers.2008/msg01264.html

>> Only if you already know DNSSEC mechanisms exist and they haven't been
>> filtered.
> 
> You can't filter DNSSEC mechanisms without that filtration being
> detected (on a validating resolver).
> 
> This includes the ability to determine whether DNSSEC mechanisms exist.
> 
> (The above is predicated on some configured trust anchor, either a
> signed root or via locally configured trust anchors, or DLV.)

That was my point, you have to know about it already one way or another
for it to work, otherwise it can simply be ignored by upstream caching
servers.

> BTW - critical analysis of DNSSEC and alternatives is by no means
> discouraged, and I think any time anyone brings fresh eyes to the
> problem, only good things can come of it - if polite, reasoned discourse
> is the result.

Again I apologise if I've said anything that unduly offended anyone, I'm
merely expressing my opinions based on what I know about certain topics
and I may have made incorrect assumptions and I'm only too happy to be
corrected so I don't make the same mistakes in future.

-- 

Best regards,
 Duane

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From: Duane <duane@e164.org>
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To: Mark Andrews <Mark_Andrews@isc.org>
CC: Paul Vixie <vixie@isc.org>, Olaf Kolkman <olaf@NLnetLabs.nl>, 
 bert hubert <bert.hubert@netherlabs.nl>,
 Namedroppers <namedroppers@ops.ietf.org>
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
References: <200808080452.m784q46m007017@drugs.dv.isc.org>
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Mark Andrews wrote:

> People setup caching servers everyday today.  Setting up one to
> also do validation is not that much extra.  

Most people don't, the ones that do can probably do as you suggest, but
in reality the ones that would most benefit are those that rely on ISPs
or their routers/modems to do it all for them.

> And education is the solution to that.

That only works if people are interested in the learning you are trying
to impart to them. Most people will be complacent about such matters
until it really really matters to them personally. Such as loosing money
to an internet scam.

> People aren't as stupid as we often portray then as.  Give them
> good information and they will use it.  Do best practice from the
> start.

I'm not commenting on people's intelligence, I should have made my point
clearer I suppose, a general apathy plus some ignorance of the
mechanisms of how computers work and people don't care to learn beyond
that, until they have to and well by then it's usually too late the
horse has already bolted and they do the whole talk show scene trying to
get everyone to learn from their mistakes, which for the most part most
people don't.

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 23:02:08 2008
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Subject: The problem I see with DNSSEC as a potential end user and administrator.
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I just spoke to Mark on the phone, I'm sure he'll have some interesting
remarks about that in private, but to sum things up the conclusion I was
trying (poorly) to get across to Mark was this.

The higher the perceived cost, and the lower the perceived benefit will
make people complacent about deploying DNSSEC.

If the PDF link Bert posted is anything to go by there is a long way to
go before it's simple enough for people not to care about doing 1 or 2
things extra to implement DNSSEC.

However while ever the process is so long and drawn out, regardless of
how much worst it was in the past, people won't be bothered with it
until or unless they are personally effected in some respect.

You can't over come complacency by saying the process is simpler now
then it used to be and how easy it is to setup, it doesn't wash with me
or anyone else like me. We all live busy lives and all have better
things to do then care about if the zone is signed or not at present
because of a lack of tangible benefit.

Further more when anything gets more complicated I worry about how much
additional maintenance work it will take putting out fires in the future
when something breaks. Something always breaks so it isn't a matter of
if but when.

To sum things up, I don't care how easy the people promoting DNSSEC is,
it is still much too drawn out and I have better things to do with my
time then doing a bunch on mundane and repetitive things which computers
are so much better at.

Make the setup so easy a cave man could do it, or even better, fully
automate then when there is no perceived additional cost people will
start adopting it.

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 23:05:00 2008
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 Namedroppers <namedroppers@ops.ietf.org>
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
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Duane wrote:
> Mark Andrews wrote:
>
>   
>> 	Well we could stop caching any DNS data.  That's the only
>> 	way to make it match the credit card industry model where
>> 	changes are instantly available.
>>     
>
> Anyone have any idea how many credit card transactions per second occur?
>
>   

Ballpark figure - 6.5 B people, 10 transactions per day average, gives ~ 
1M/s worldwide.

There are about 1.5M unique hosts seen at the root and TLD servers per 
day, most are caching resolvers.

If the rates were comparable, each resolver would process ~ 1 
query/second. Off by several orders of magnitude.

> Seems to me they are very similar in topology, so even if you only
> cached information for a small amount of time that would mitigate most
> attacks people seem to be so concerned about at present.
>
>   

Sorry, the details on the attack methods and vectors means you would 
throw away good answers more often
than you would throw away bad answers (from the cache), but an empty 
cache for a given domain is an extra vector.

Long TTLs are your friend. That those happen to benefit scaling is a 
bonus, not an assumption.

Here's a clue - credit card transactions are in effect only signed in 
real-time, not processed per se.
The actual transactions are still batch processed much later.
This is in part to avoid data leakage through the authentication process 
itself.

So, DNSSEC is already pretty similar to CC's, just with better scaling 
properties and less overhead.

> Since the window of opportunity for these sort of attacks would be
> greatly reduced, the cost to commit these types of attacks would greatly
> increase if not be virtually impossible to commit on any kind of scale
> worth doing, so problem solved.
>
>   
Not.

Brian


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From owner-namedroppers@ops.ietf.org  Thu Aug  7 23:29:11 2008
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 Paul Vixie <paul@vix.com>, bert hubert <bert.hubert@netherlabs.nl>
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Duane,

Can we get a last name please? We already have one Duane on this list 
and it's hard to know who you are.  Is that too much to ask?  This is an 
IETF mailing list, after all.

-David

Duane wrote:
> I just spoke to Mark on the phone, I'm sure he'll have some interesting
> remarks about that in private, but to sum things up the conclusion I was
> trying (poorly) to get across to Mark was this.
> 
> The higher the perceived cost, and the lower the perceived benefit will
> make people complacent about deploying DNSSEC.
> 
> If the PDF link Bert posted is anything to go by there is a long way to
> go before it's simple enough for people not to care about doing 1 or 2
> things extra to implement DNSSEC.
> 
> However while ever the process is so long and drawn out, regardless of
> how much worst it was in the past, people won't be bothered with it
> until or unless they are personally effected in some respect.
> 
> You can't over come complacency by saying the process is simpler now
> then it used to be and how easy it is to setup, it doesn't wash with me
> or anyone else like me. We all live busy lives and all have better
> things to do then care about if the zone is signed or not at present
> because of a lack of tangible benefit.
> 
> Further more when anything gets more complicated I worry about how much
> additional maintenance work it will take putting out fires in the future
> when something breaks. Something always breaks so it isn't a matter of
> if but when.
> 
> To sum things up, I don't care how easy the people promoting DNSSEC is,
> it is still much too drawn out and I have better things to do with my
> time then doing a bunch on mundane and repetitive things which computers
> are so much better at.
> 
> Make the setup so easy a cave man could do it, or even better, fully
> automate then when there is no perceived additional cost people will
> start adopting it.
> 


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Wouter Wijngaards wrote:

> A new version of my resolver (Unbound) with additional filtering of
> responses to counter the recently disclosed vulnerability at blackhat
> was just released. This filtering is in addition to the bailiwick
> checking.

No.

If you properly handle additional glue As to be tagged by query,
glue As does not need any bailiwick checking.

As answer non-glue additional information needs exact matching with
query, the information needs no bailiwick checking.

"Bailiwick" was considered to be a valid concept for non-glue
information but is never a valid concept for glue-As.

No WG consensus can override scientific nature of the DNS referral
mechanism.

> The best solution is of course DNSSEC.

A better solution, a lot more easier to deploy than DNSSEC, is to
use TCP, deployment of which is, of course, still hard.

However, it is only as hard as updating all the install bases,
including those on various types of NAT boxed, of DNS so that
they can treat glue and other information properly.

> Crypto signatures instead of randomisation games. Enable DNSSEC
> validation now.

Because of complexity of DNSSEC caused by poor combination of DNS
and public key cryptography, there are a several subtle hacking,
which are not present in PODS (plain old DNS), performed to make
it work.

With such additional subtlities, it is practically impossible to
be sure that DNSSEC is more secure than PODS.

Remember that even PODS has a lot of unexpected security
holes.

							Masataka Ohta


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Brian Dickson wrote:

> Ballpark figure - 6.5 B people, 10 transactions per day average, gives ~
> 1M/s worldwide.
> If the rates were comparable, each resolver would process ~ 1
> query/second. Off by several orders of magnitude.

So you are stating there is more CC authorisations per second for CC's
than DNS, and if that system works so well (most of the time) why can't
DNS follow that approach too?

> Sorry, the details on the attack methods and vectors means you would
> throw away good answers more often
> than you would throw away bad answers (from the cache), but an empty
> cache for a given domain is an extra vector.

Very few ISPs cache websites any more even though there is tangible
benefits in doing so still, but due to a variety of reasons many stopped
doing caching because it was more hassle then it was worth, at present
for me and others DNSSEC is more hassle then it's worth.

In short web pages could be cached rather than 'throw' away good answers
but they don't, why should caching DNS be given any more consideration
in this respect?

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Thu Aug  7 23:43:39 2008
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David Ulevitch wrote:
> Duane,
> 
> Can we get a last name please? We already have one Duane on this list
> and it's hard to know who you are.  Is that too much to ask?  This is an
> IETF mailing list, after all.

In all the time I've used the internet you are the only person to care
at all.

-- 

Best regards,
 Duane

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 Wouter Wijngaards <wouter@NLnetLabs.nl>
Subject: Re: Additional filtering of responses
References: <489AD5E3.20708@nlnetlabs.nl> <45759.1218122552@nsa.vix.com> <OF8C6AC1F0.001ADC24-ON8025749E.00576A89-C125749E.005ADCE2@nominet.org.uk>
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Roy Arends wrote:

> ;; ->>HEADER<<- opcode: QUERY, status: NOERROR, id: 37612
> ;; flags: qr aa; QUERY: 1, ANSWER: 1, AUTHORITY: 1, ADDITIONAL: 0
> 
> ;; QUESTION SECTION:
> ;010a.example.          IN      A
> 
> ;; ANSWER SECTION:
> 010a.example.           86400   IN      A       192.0.2.9
> 
> ;; AUTHORITY SECTION:
> example.                86400   IN      NS      010a.example.
> 
> ;; Query time: 3 msec
> ;; SERVER: 192.0.2.10#53(192.0.2.10)
> 
> No glue. No additional section. 
> 
> Is the address record in the answer section cached? 
> When cached, is 192.0.2.9 considered authoritative now for future lookups 
> under example?

It seems to me that referral NSes should also be cached tagged by
the query domain, which means 010a.example will be authoritative
for future lookups on 010a.example but nothing else.

						Masataka Ohta


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Masataka Ohta <mohta@necom830.hpcl.titech.ac.jp> wrote on 08/08/2008 
08:50:57 AM:

> Roy Arends wrote:
> 
> > ;; ->>HEADER<<- opcode: QUERY, status: NOERROR, id: 37612
> > ;; flags: qr aa; QUERY: 1, ANSWER: 1, AUTHORITY: 1, ADDITIONAL: 0
> > 
> > ;; QUESTION SECTION:
> > ;010a.example.          IN      A
> > 
> > ;; ANSWER SECTION:
> > 010a.example.           86400   IN      A       192.0.2.9
> > 
> > ;; AUTHORITY SECTION:
> > example.                86400   IN      NS      010a.example.
> > 
> > ;; Query time: 3 msec
> > ;; SERVER: 192.0.2.10#53(192.0.2.10)
> > 
> > No glue. No additional section. 
> > 
> > Is the address record in the answer section cached? 
> > When cached, is 192.0.2.9 considered authoritative now for future 
lookups 
> > under example?
> 
> It seems to me that referral NSes should also be cached tagged by
> the query domain, which means 010a.example will be authoritative
> for future lookups on 010a.example but nothing else.

Okay.

Where does the resolver get the address to go for lookups (other than 
010a.example) under example ?

Thanks

Roy

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From owner-namedroppers@ops.ietf.org  Fri Aug  8 00:08:41 2008
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From: Ralf Weber <denic@eng.colt.net>
To: bert hubert <bert.hubert@netherlabs.nl>,
	Namedroppers <namedroppers@ops.ietf.org>
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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
Date: Fri, 8 Aug 2008 09:05:04 +0200
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Moin!

On Aug 7, 2008, at 15:42 , bert hubert wrote:

> On Thu, Aug 07, 2008 at 01:00:51PM +0200, Wouter Wijngaards wrote:
>> The best solution is of course DNSSEC. Crypto signatures instead of
>> randomisation games. Enable DNSSEC validation now.
>
> Not specifically aimed at you Wouter, but it appears the most vocal =20=

> people
> in the DNS world are starting to suffer from "groupthink".
Ok so let me state my opinion as someone who argued against DNSSEC =20
until last year hopefully does not fall into the "groupthink" theory.

The reason it changed is that we, or to be more precise a customer was =20=

hit by cache poisoning, and I had show up at there board and explain =20
it to them.

So there question was and I raise it to the WG here:
Is there a technology that can prove that the answer I am getting from =20=

my DNS resolver is correct?
To my limited knowledge the only answer to the above question is:
Yes DNSSEC can do this.
But please tell me if you know another solution.

All other solutions proposed here so far only lower the chance of an =20
attacker to poison the cache. But still with a 0.0001% chance the =20
attacker might just have that lucky packet and poison your cache. So =20
why I think it is good to do countermeasures none of them can assure =20
me that I won't be hit by cache poisoning.

Also as stated elsewhere here, if someone today wanted to secure DNS =20
between him and his business partners he could do it today without =20
involving anyone else but him and the business partners (and this is =20
happening).

Now having played around with DNSSEC for a year now I also must say =20
that it does it's job, but with the current software and tools =20
available it's simply not ready for widespread adoption. But this is a =20=

problem that can be solved, there is IMHO nothing wrong with the =20
protocol, it's the tools that don't offer a user friendly way to =20
deploy it.

So people should focus on getting the tools right.

So long
-Ralf
---
Ralf Weber
Platform Infrastructure Manager
Colt Telecom GmbH
Herriotstrasse 4
60528 Frankfurt
Germany
DDI: +49 (0)69 56606 2780 Internal OneDial: 8 491 2780
Fax: +49 (0)69 56606 6280
Email: Ralf.Weber@colt.net
http://www.colt.net/

Data | Voice | Managed Services

*****************************************
COLT Telecom GmbH, Herriotstra=DFe 4, 60528 Frankfurt/Main, Deutschland =
*
Tel +49 (0)69 56606 0 * Fax +49 (0)69 56606 2222 *
Gesch=E4ftsf=FChrer: Albertus Marinus Oosterom (Vors.), Rita Thies *
Amtsgericht Frankfurt/Main HRB 53898 * USt.-IdNr. DE 220 772 475



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From owner-namedroppers@ops.ietf.org  Fri Aug  8 00:18:36 2008
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Roy Arends wrote:

> Where does the resolver get the address to go for lookups (other than 
> 010a.example) under example ?

Root nameservers, I'm afraid.

							Masataka Ohta


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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
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Ralf Weber wrote:

> The reason it changed is that we, or to be more precise a customer was
> hit by cache poisoning, and I had show up at there board and explain it
> to them.

Thanks for proving my point, people won't do anything until something
happens to them personally.

> Is there a technology that can prove that the answer I am getting from my DNS resolver is correct? 

Don't use someone else's resolver for starters, then reduce the TTL to
almost nothing and the chance of being effected is greatly reduced, of
course DNSSEC won't solve this problem without critical mass either so
even if you deploy or utilise DNSSEC you could still be effected by
cache poisoning.

-- 

Best regards,
 Duane

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Subject: Re: Additional filtering of responses
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Masataka Ohta wrote:
> Roy Arends wrote:
> 
>> Where does the resolver get the address to go for lookups (other than 
>> 010a.example) under example ?
> 
> Root nameservers, I'm afraid.

Oh so this is what Verisign had in mind when they announced they were
ramping up DNS response capabilities by 10 or 100 fold.

-- 

Best regards,
 Duane

http://www.freeauth.org - Enterprise Two Factor Authentication
http://www.nodedb.com - Think globally, network locally
http://www.sydneywireless.com - Telecommunications Freedom
http://e164.org - Global Communication for the 21st Century

"In the long run the pessimist may be proved right,
    but the optimist has a better time on the trip."

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From: Ralf Weber <denic@eng.colt.net>
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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
Date: Fri, 8 Aug 2008 09:43:42 +0200
References: <489AD5E3.20708@nlnetlabs.nl> <20080807134236.GA19024@outpost.ds9a.nl> <E3BF6308-12F6-4269-B949-2853E5E8F607@eng.colt.net> <489BF4C8.9000309@e164.org>
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Moin!

On Aug 8, 2008, at 09:24 , Duane at e164 dot org wrote:

> Ralf Weber wrote:
>
>> The reason it changed is that we, or to be more precise a customer =20=

>> was
>> hit by cache poisoning, and I had show up at there board and =20
>> explain it
>> to them.
>
> Thanks for proving my point, people won't do anything until something
> happens to them personally.
Well this might happen more often now when the hackers do code that =20
utilises Dan Kaminskys findings. And it just need to happen to the =20
"right" people, as we see with IPv6 now that which is at least getting =20=

some traction after governments endorsed it.

>> Is there a technology that can prove that the answer I am getting =20
>> from my DNS resolver is correct?
>
> Don't use someone else's resolver for starters,
Hmm shall I stop offering resolving service to our customers, so that =20=

they can have their own ;-).

> then reduce the TTL to
> almost nothing and the chance of being effected is greatly reduced, of
> course DNSSEC won't solve this problem without critical mass either so
> even if you deploy or utilise DNSSEC you could still be effected by
> cache poisoning.
True, but if A and B agree on using it they can at least secure the =20
resolving of A and Bs domains, and if C, D and E join them when a TLD =20=

operator offers DNSSEC domains they will be also secured. So it will =20
get better the more people do it, and the of non DNSSEC servers to =20
speak to DNSSEC servers is at least defined (unless IPv6).

So long
-Ralf
---
Ralf Weber
Platform Infrastructure Manager
Colt Telecom GmbH
Herriotstrasse 4
60528 Frankfurt
Germany
DDI: +49 (0)69 56606 2780 Internal OneDial: 8 491 2780
Fax: +49 (0)69 56606 6280
Email: Ralf.Weber@colt.net
http://www.colt.net/

Data | Voice | Managed Services

*****************************************
COLT Telecom GmbH, Herriotstra=DFe 4, 60528 Frankfurt/Main, Deutschland =
*
Tel +49 (0)69 56606 0 * Fax +49 (0)69 56606 2222 *
Gesch=E4ftsf=FChrer: Albertus Marinus Oosterom (Vors.), Rita Thies *
Amtsgericht Frankfurt/Main HRB 53898 * USt.-IdNr. DE 220 772 475



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From owner-namedroppers@ops.ietf.org  Fri Aug  8 00:56:06 2008
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--On 8 August 2008 17:24:56 +1000 Duane at e164 dot org <duane@e164.org> 
wrote:

>> Is there a technology that can prove that the answer I am getting from
>> my DNS resolver is correct?
>
> Don't use someone else's resolver for starters, then reduce the TTL to
> almost nothing and the chance of being effected is greatly reduced, of
> course DNSSEC won't solve this problem without critical mass either so
> even if you deploy or utilise DNSSEC you could still be effected by
> cache poisoning.

That just goes to prove Ralf's point.
a) DNSSEC may be an ugly pig, but it's the only technology available today
   that PROVES the answer is correct (rather than 'greatly reduces' the
   chance of it being wrong)
b) Like most security measures, both sides need to be using it. It does
   little in practice at the moment because it isn't deployed (no critical
   mass, as you put it). This is not an argument not to deploy it
   ("my gun does not work because it is not loaded, therefore do not load
   it because it does not work"); if anything, it's the opposite.

Alex

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To: Masataka Ohta <mohta@necom830.hpcl.titech.ac.jp>
Cc: Paul Vixie <vixie@isc.org>,  namedroppers@ops.ietf.org
Subject: Re: correction! Re: The math of RFC3833.2.2-spoofing a randomising source port resolver
References: <20080801124038.GA5994@outpost.ds9a.nl>
	<20080804104502.GA32568@outpost.ds9a.nl>
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From: Florian Weimer <fweimer@bfk.de>
Date: Fri, 08 Aug 2008 09:59:51 +0200
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* Masataka Ohta:

>> Or you cache referrals without storing any name server name.
>> Conceptually, this seems to be the much simpler approach.
>
> If you mean the cached referral is tagged with the original query,
> the complexity is no different from mine.

No, after detecting a referral, you record the addresses in the
additional section and store it at the name of the zone.  You don't
associate it with any name server names.  This means that the data can
only be used for this referral, and nowhere else.

This prevents cache insertion through glue records.  You can even use
address information from out-of-zone glue to locate servers (provided
that the upstream server filters out-of-zone data properly, which is
probably something you cannot assume).

> Paul Vixie wrote:
>
>> i don't think so, since nameservers can be renumbered without being
>> renamed.
>
> TTL, which must be properly configured by zone administrators, takes
> care of it.

Agreed.

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=DFe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
References: <489AD5E3.20708@nlnetlabs.nl> <20080807134236.GA19024@outpost.ds9a.nl> <E3BF6308-12F6-4269-B949-2853E5E8F607@eng.colt.net> <489BF4C8.9000309@e164.org> <B786FB32-89AB-412E-A502-1CEB9A404041@eng.colt.net>
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Ralf Weber wrote:

> Well this might happen more often now when the hackers do code that
> utilises Dan Kaminskys findings. And it just need to happen to the
> "right" people, as we see with IPv6 now that which is at least getting
> some traction after governments endorsed it.

Either that or they all migrated to recursors that weren't affected and
so that would mitigate any migration to DNSSEC.

-- 

Best regards,
 Duane

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To: Alex Bligh <alex@alex.org.uk>
CC: Ralf Weber <denic@eng.colt.net>, 
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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
References: <489AD5E3.20708@nlnetlabs.nl> <20080807134236.GA19024@outpost.ds9a.nl> <E3BF6308-12F6-4269-B949-2853E5E8F607@eng.colt.net> <489BF4C8.9000309@e164.org> <09B9BDC1BA78A4C82CC20893@nimrod.local>
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Alex Bligh wrote:

Ignore the fact of what DNSSEC can do, ignore even what it can't do, the
bigger hurdle to getting most people to deploy it will be the ease at
which they can set it up, other external factors will occur that may
change the rate of deployment but why people aren't actively trying to
make the process as simple as possible is beyond me.

--=20

Best regards,
 Duane


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From owner-namedroppers@ops.ietf.org  Fri Aug  8 01:56:22 2008
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To: duane@e164.org
Cc: denic@eng.colt.net, bert.hubert@netherlabs.nl, namedroppers@ops.ietf.org
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
From: sthaug@nethelp.no
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> > Well this might happen more often now when the hackers do code that
> > utilises Dan Kaminskys findings. And it just need to happen to the
> > "right" people, as we see with IPv6 now that which is at least getting
> > some traction after governments endorsed it.
> 
> Either that or they all migrated to recursors that weren't affected and
> so that would mitigate any migration to DNSSEC.

Your "recursors that weren't affected" don't exist. Using more entropy
(by using query ID randomization, port randomzation etc) reduces the
probability of spoofing - but as has been pointed out many times here,
this is not a *solution*. It mitigates the problem, it doesn't solve
it.

Steinar Haug, Nethelp consulting, sthaug@nethelp.no

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From owner-namedroppers@ops.ietf.org  Fri Aug  8 01:58:34 2008
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From: bert hubert <bert.hubert@netherlabs.nl>
To: sthaug@nethelp.no
Cc: duane@e164.org, denic@eng.colt.net, namedroppers@ops.ietf.org
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
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References: <489BF4C8.9000309@e164.org> <B786FB32-89AB-412E-A502-1CEB9A404041@eng.colt.net> <489C0370.4080502@e164.org> <20080808.104957.74720707.sthaug@nethelp.no>
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On Fri, Aug 08, 2008 at 10:49:57AM +0200, sthaug@nethelp.no wrote:

> probability of spoofing - but as has been pointed out many times here,
> this is not a *solution*. It mitigates the problem, it doesn't solve
> it.

Mitigation to the point where it will take a million years is effectively a
solution against spoofing.

People with sufficiently powerful computers could also break DNSSEC
security. 

This is equally likely to take a million years, although I haven't studied
the effective keylenghts that fit in DNS.

I'll repeat the mantra that DNSSEC protects against more than spoofing.

	Bert

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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From owner-namedroppers@ops.ietf.org  Fri Aug  8 02:17:34 2008
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CC: Namedroppers <namedroppers@ops.ietf.org>, 
 Mark Andrews <Mark_Andrews@isc.org>,
 Paul Vixie <paul@vix.com>, bert hubert <bert.hubert@netherlabs.nl>
Subject: Re: The problem I see with DNSSEC as a potential end user and administrator.
References: <489BE047.1010100@e164.org> <e90946380808080203g65c99a72meca9db15c1194df1@mail.gmail.com>
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Ond=C5=99ej Sur=C3=BD wrote:

> I know that it does add more burder of shoulder of any sysadmin, but
> is it really so much - add a cron job and some monitoring script and
> you are done?

at some point you load the beasts of burden up with so much work that
one extra piece of straw is all that is needed or takes to break the
poor animals back.

--=20

Best regards,
 Duane


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From: "=?UTF-8?Q?Ond=C5=99ej_Sur=C3=BD?=" <ondrej.sury@nic.cz>
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Subject: Re: The problem I see with DNSSEC as a potential end user and administrator.
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From owner-namedroppers@ops.ietf.org  Fri Aug  8 02:31:02 2008
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Subject: Re: The problem I see with DNSSEC as a potential end user and administrator.
References: <489BE047.1010100@e164.org>	 <e90946380808080203g65c99a72meca9db15c1194df1@mail.gmail.com>	 <489C0E08.3040406@e164.org> <e90946380808080218n7acddd46gd99d39fa71edcb26@mail.gmail.com>
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Ond=C5=99ej Sur=C3=BD wrote:
> 2008/8/8 Duane at e164 dot org <duane@e164.org>:
>> Ond=C5=99ej Sur=C3=BD wrote:
>>
>>> I know that it does add more burder of shoulder of any sysadmin, but
>>> is it really so much - add a cron job and some monitoring script and
>>> you are done?
>> at some point you load the beasts of burden up with so much work that
>> one extra piece of straw is all that is needed or takes to break the
>> poor animals back.
>=20
> But now is starts to be only rhethorical discussion.  Have you calculat=
ed
> how much additional work it would be for you?  Using right tools for it=

> (like dnssec-tools[1] or ZKT[2])?

If I have to go out of my way to learn about this stuff you again have
shown it is neither straight forward nor simple to do.

Until I can type a single command (or no commands) that sets everything
up I really can't be bothered, since there is no perceived benefit in
doing so for me.

--=20

Best regards,
 Duane


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From owner-namedroppers@ops.ietf.org  Fri Aug  8 02:34:03 2008
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From: Duane at e164 dot org <duane@e164.org>
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To: bert hubert <bert.hubert@netherlabs.nl>
CC: sthaug@nethelp.no, denic@eng.colt.net, namedroppers@ops.ietf.org
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
References: <489BF4C8.9000309@e164.org> <B786FB32-89AB-412E-A502-1CEB9A404041@eng.colt.net> <489C0370.4080502@e164.org> <20080808.104957.74720707.sthaug@nethelp.no> <20080808085430.GC6566@outpost.ds9a.nl>
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bert hubert wrote:
> On Fri, Aug 08, 2008 at 10:49:57AM +0200, sthaug@nethelp.no wrote:
> 
>> probability of spoofing - but as has been pointed out many times here,
>> this is not a *solution*. It mitigates the problem, it doesn't solve
>> it.
> 
> Mitigation to the point where it will take a million years is effectively a
> solution against spoofing.
> 
> People with sufficiently powerful computers could also break DNSSEC
> security. 

Or knowledge to factor asymmetric keys in a way no one else has thought
of would be able to perpetrate a DNSSEC attack much easier again.

Currently it's assumed that quantum computing would be needed to solve
this problem, however people assumed md5/sha1 didn't suffer any flaws
until it came out they were vulnerable.

Brute force is merely the slowest way to break keys, not the only way.

As for CPU hours needed to brute force keys:

http://en.wikipedia.org/wiki/RSA_Factoring_Challenge

A tad less than a million ;)

-- 

Best regards,
 Duane

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From: "=?UTF-8?Q?Ond=C5=99ej_Sur=C3=BD?=" <ondrej.sury@nic.cz>
To: "Duane at e164 dot org" <duane@e164.org>
Subject: Re: The problem I see with DNSSEC as a potential end user and administrator.
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From: Duane at e164 dot org <duane@e164.org>
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CC: Namedroppers <namedroppers@ops.ietf.org>, 
 Mark Andrews <Mark_Andrews@isc.org>,
 Paul Vixie <paul@vix.com>, bert hubert <bert.hubert@netherlabs.nl>
Subject: Re: The problem I see with DNSSEC as a potential end user and administrator.
References: <489BE047.1010100@e164.org>	 <e90946380808080203g65c99a72meca9db15c1194df1@mail.gmail.com>	 <489C0E08.3040406@e164.org>	 <e90946380808080218n7acddd46gd99d39fa71edcb26@mail.gmail.com>	 <489C112A.8000306@e164.org> <e90946380808080232w756e1123u2237fa1ac846173f@mail.gmail.com>
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Ond=C5=99ej Sur=C3=BD wrote:

> So when you installed your DNS server infrastructure, was it just
> some "magic" command which caused all your domain names to be server
> by that servers?  Or did you have to make changes to config files,
> generate TSIG keys, configure primary, configure slaves, add zones
> to config file...

apt-get scripts either prompt for more information or pre-config nearly
everything out of the box.

> I see kind of analogy here.  Available tools are bit rough at this time=
,
> but it's magnituted better that it was half a year ago.

What was, is meaningless to those that don't know or care, what is, is
all that matters if you are trying to sell DNSSEC to the unwashed masses
that aren't drinking the koolaid.

--=20

Best regards,
 Duane


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From: Peter Koch <pk@DENIC.DE>
To: IETF DNSEXT WG <namedroppers@ops.ietf.org>
Subject: Re: Additional filtering of responses
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On Thu, Aug 07, 2008 at 06:32:35PM +0200, Roy Arends wrote:

> ;; ->>HEADER<<- opcode: QUERY, status: NOERROR, id: 37612
> ;; flags: qr aa; QUERY: 1, ANSWER: 1, AUTHORITY: 1, ADDITIONAL: 0

note: neither RD nor RA, so this is a response from an authoritative
server.

> ;; QUESTION SECTION:
> ;010a.example.          IN      A
> 
> ;; ANSWER SECTION:
> 010a.example.           86400   IN      A       192.0.2.9
> 
> ;; AUTHORITY SECTION:
> example.                86400   IN      NS      010a.example.
> 
> ;; Query time: 3 msec
> ;; SERVER: 192.0.2.10#53(192.0.2.10)
> 
> No glue. No additional section. 

There's nothing to glue here anyway.

> Is the address record in the answer section cached? 
> When cached, is 192.0.2.9 considered authoritative now for future lookups 
> under example? 

The question is whether "recursive servers" should continue to believe
the NS RRSet in the authority section more than what they had learned
by referral.  Insofar your question has two parts:
1) should the NS RR in the authority section be used for further lookups
   within the example domain?
2) If "yes" or the referral already had the same data, should "192.0.2.9"
   be used as an address no matter what the referral had provided as
   additional information (and, this time, originating from glue)?

If you say "no" to the first question, given all the parent/child
inconsistencies, I'd be scared by the operational effects of such a paradigm
shift.

> Will that NS record ever expire if a query is send once a day ?

This question of "auth server lock in" has been brought up by Antoin a
couple of times and is probably independent of the current discussion.
We know it "should not happen".

-Peter

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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
References: <489AD5E3.20708@nlnetlabs.nl>	 <20080807134236.GA19024@outpost.ds9a.nl>	 <E3BF6308-12F6-4269-B949-2853E5E8F607@eng.colt.net>	 <489BF4C8.9000309@e164.org>	 <e90946380808080214w431d9298rf819b8b96c7fca3f@mail.gmail.com> <e90946380808080215v2f8e25a8pffe0b9ddb308daab@mail.gmail.com>
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Ond=C5=99ej Sur=C3=BD wrote:

> Did you imagined how would this impact root and tld servers (well and
> registrars and others) servers
> if everybody would do this?

I highly doubt everyone will do this, then again everyone keeps going on
about end to end verification and the end user talking directly to
authority name servers would get rid of the whole issue over cache
poisoning altogether, wouldn't mitigate ISP attacks, but then again Paul
Vixie wasn't looking to fight that battle in a previous email thread.

Web caches/proxies for the most part have gone away, site owners that do
large amounts of hits didn't bemoan how bad that was, why do we still
cling to the notion that we must at all cost use DNS caches?

--=20

Best regards,
 Duane


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To: "Duane at e164 dot org" <duane@e164.org>
Subject: Re: The problem I see with DNSSEC as a potential end user and administrator.
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Subject: Re: The problem I see with DNSSEC as a potential end user and administrator.
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Ond=C5=99ej Sur=C3=BD wrote:

> Well, we don't need to sell it to masses.  We just need to educated reg=
istrars,
> ISPs and big zone hosters, where people with (at least some) clue works=
=2E
> And that's something what we are working on.

I wish you well on your endeavour, I've said my piece but so far no one
has convinced me over DNSSEC to date.

Also you are assuming I don't have anything to do with administering a
large number of zones, but that's ok :)

--=20

Best regards,
 Duane


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Subject: Re: The problem I see with DNSSEC as a potential end user and administrator.
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[This thread has gone off-topic, so has this reply]

On Aug 8, 2008, at 11:52 AM, Ond=C5=99ej Sur=C3=BD wrote:

> 2008/8/8 Duane at e164 dot org <duane@e164.org>:
>> Ond=C5=99ej Sur=C3=BD wrote:
>>
>>> So when you installed your DNS server infrastructure, was it just
>>> some "magic" command which caused all your domain names to be server
>>> by that servers?  Or did you have to make changes to config files,
>>> generate TSIG keys, configure primary, configure slaves, add zones
>>> to config file...
>>
>> apt-get scripts either prompt for more information or pre-config =20
>> nearly
>> everything out of the box.
>
> No, it doesn't.  It just add some preconfiguration for rDNS, but it =20=

> doesn't
> setup your zones.  You have to add them manually.  Same with TSIG, =20
> slaves,
> etc.
>
>>> I see kind of analogy here.  Available tools are bit rough at this =20=

>>> time,
>>> but it's magnituted better that it was half a year ago.
>>
>> What was, is meaningless to those that don't know or care, what is, =20=

>> is
>> all that matters if you are trying to sell DNSSEC to the unwashed =20
>> masses
>> that aren't drinking the koolaid.
>
> Well, we don't need to sell it to masses.  We just need to educated =20=

> registrars,
> ISPs and big zone hosters, where people with (at least some) clue =20
> works.
> And that's something what we are working on.




Ond=C5=99ej Sur=C3=BD, Duane Groth,

You are both right.

We need the clueful folk to deploy and provide basic infrastructure, =20
we need the clueful folk to build the tools, the devices and auto-=20
scripts, and then we need the masses to make deployment a success. We =20=

are still at the beginning of the deployment curve.

But mind you. If you want to do DNSSEC in a no-brain fashion there are =20=

proprietary solutions already (just like there are proprietary =20
solutions for plain-old DNSSEC management).

The design of management software is to a great extend off-topic for =20
this list, unless we need protocols to make them interoperate.

We have RFC5011 to manage part of that (open-source implementation =20
forthcoming) and numerous folk are working on key-maintenance tools. =20
See for instance: http://www.dnssec-tools/, http://=20
www.opendnssec.org/, http://www.xtcn.com/ lamb/pkcs11HSMtools.tar.gz, =20=

and http://www.ripe.net/disi/dnssec_maint_tool/ are some initiatives I =20=

am aware of. ISC has announced work on tools for the next version of =20
bind.

I would agree with claims that most of them are far from state-of the =20=

art, but the activity in this area is rapidly increasing.

Duane , you seem to be the kind of guy that knows both what end-users =20=

really need, and have the clue to spec and implement that ;-)

--Olaf

PS. I will keep an open eye on alternative protocol or operational =20
practices that will help to bridge the gap between now and the time =20
that DNSSEC has seen sufficient deployment to make it useful, but I =20
will try to refrain from entering in future off-topic debates on this =20=

issue on this list.


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On Fri, Aug 08, 2008 at 11:52:08AM +0200, Ond??ej Surý wrote:
> > What was, is meaningless to those that don't know or care, what is, is
> > all that matters if you are trying to sell DNSSEC to the unwashed masses
> > that aren't drinking the koolaid.
> 
> Well, we don't need to sell it to masses.  We just need to educated registrars,
> ISPs and big zone hosters, where people with (at least some) clue works.
> And that's something what we are working on.

If you don't deploy it to a hundred percent it simply won't be 'the solution'
to the spoofing and man-in-the-middle problem as some people here like to
think. Saturation is important to the success of a protocol, think of blueray
vs. hd-dvd so you need not only to address the forbes500 but also
www.mylittlewebsitethatsellsstuff.cctld, that kind of thing is often run by
small companys that lack the clue you want people to have.

	Stefan
-- 
There is hopeful symbolism in the fact that flags don't wave in a vacuum.
- Arthur C. Clark 

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In-Reply-To: <e90946380808080252r35e88807v15e904d10c73cb76@mail.gmail.com>
Subject: Re: The problem I see with DNSSEC as a potential end user and administrator.
References: <489BE047.1010100@e164.org> <e90946380808080203g65c99a72meca9db15c1194df1@mail.gmail.com> <489C0E08.3040406@e164.org> <e90946380808080218n7acddd46gd99d39fa71edcb26@mail.gmail.com> <489C112A.8000306@e164.org> <e90946380808080232w756e1123u2237fa1ac846173f@mail.gmail.com> <489C140C.60205@e164.org> <e90946380808080252r35e88807v15e904d10c73cb76@mail.gmail.com>
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Date: Fri, 8 Aug 2008 12:31:41 +0200
Cc: "Duane at e164 dot org" <duane@e164.org>,
	Namedroppers <namedroppers@ops.ietf.org>,
	"Mark Andrews" <Mark_Andrews@isc.org>, "Paul Vixie" <paul@vix.com>,
	"bert hubert" <bert.hubert@netherlabs.nl>
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Moin!

On Aug 8, 2008, at 11:52 , Ond=C5=99ej Sur=C3=BD wrote:
> Well, we don't need to sell it to masses.  We just need to educated =20=

> registrars,
> ISPs and big zone hosters, where people with (at least some) clue =20
> works.
Well even these guys (I think my company is in one of the above =20
mentioned business ;-) want tools that don't put to much operational =20
burden on them. So a switch or checkbox that says DNSSEC enabled for =20
that zone, and does all the rest in background (KSK, ZSK generation, =20
zone signing and resigning, ZSK rollover, KSK rollover) is something =20
that we  and I guess others want. Ok for KSK it would be good if it =20
offer to access it via an external storage that you only attach to the =20=

box at certain times to not have always on the box and at risk being =20
compromised. And we do want it in an integrated manner and not as a =20
bunch of different toolsets that you can stick together.

So far I know of no solution that does offer that, but if anyone knows =20=

tell me.

> And that's something what we are working on.
You can try, but I guess you will have problems when the operational =20
overhead is bigger than the potential benefit.

So long
-Ralf
---
Ralf Weber
Platform Infrastructure Manager
Colt Telecom GmbH
Herriotstrasse 4
60528 Frankfurt
Germany
DDI: +49 (0)69 56606 2780 Internal OneDial: 8 491 2780
Fax: +49 (0)69 56606 6280
Email: Ralf.Weber@colt.net
http://www.colt.net/

Data | Voice | Managed Services

*****************************************
COLT Telecom GmbH, Herriotstra=C3=9Fe 4, 60528 Frankfurt/Main, =
Deutschland *
Tel +49 (0)69 56606 0 * Fax +49 (0)69 56606 2222 *
Gesch=C3=A4ftsf=C3=BChrer: Albertus Marinus Oosterom (Vors.), Rita Thies =
*
Amtsgericht Frankfurt/Main HRB 53898 * USt.-IdNr. DE 220 772 475



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From owner-namedroppers@ops.ietf.org  Fri Aug  8 03:53:24 2008
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From: Duane at e164 dot org <duane@e164.org>
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To: Stefan Schmidt <zaphodb@zaphods.net>
CC: Namedroppers <namedroppers@ops.ietf.org>
Subject: Re: The problem I see with DNSSEC as a potential end user and	administrator.
References: <489BE047.1010100@e164.org> <e90946380808080203g65c99a72meca9db15c1194df1@mail.gmail.com> <489C0E08.3040406@e164.org> <e90946380808080218n7acddd46gd99d39fa71edcb26@mail.gmail.com> <489C112A.8000306@e164.org> <e90946380808080232w756e1123u2237fa1ac846173f@mail.gmail.com> <489C140C.60205@e164.org> <e90946380808080252r35e88807v15e904d10c73cb76@mail.gmail.com> <20080808102132.GO18233@zaphods.net>
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Stefan Schmidt wrote:

> think. Saturation is important to the success of a protocol, think of blueray
> vs. hd-dvd so you need not only to address the forbes500 but also

Actually funny you should mention blueray, an article about it today how
it may have won the format wars but no one really cares about it because
DVDs are good enough.

Many think DNS is more or less good enough and well you get the idea.

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Fri Aug  8 04:18:29 2008
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Date: Fri, 8 Aug 2008 13:12:42 +0200
From: bert hubert <bert.hubert@netherlabs.nl>
To: namedroppers@ops.ietf.org
Subject: first succesful (lab) spoof of a fully source port randomized server reported
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http://tservice.net.ru/~s0mbre/blog//devel/networking/dns/2008_08_08

"Attack took about half of the day, i.e. a bit less than 10 hours.
 So, if you have a GigE lan, any trojaned machine can poison your DNS during
 one night... "

Congratulations are due to Evgeniy Polyakov! He includes the source of his
exploit.

In the meantime, please ponder
http://www.ops.ietf.org/lists/namedroppers/namedroppers.2008/msg01213.html

	Bert
-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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From owner-namedroppers@ops.ietf.org  Fri Aug  8 04:31:31 2008
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> http://tservice.net.ru/~s0mbre/blog//devel/networking/dns/2008_08_08
> 
> "Attack took about half of the day, i.e. a bit less than 10 hours.
>  So, if you have a GigE lan, any trojaned machine can poison your DNS during
>  one night... "
> 
> Congratulations are due to Evgeniy Polyakov! He includes the source of his
> exploit.

Interesting enough. Meanwhile, if I have a recursive name server where
the total traffic from the authoritative servers is in the range of
2 - 3 Mbps, I believe I could safely rate limit the traffic from each
individual IP (representing a possibly spoofed authoritative server) to
100 - 200 kbps. This should raise the bar somewhat.

Steinar Haug, Nethelp consulting, sthaug@nethelp.no

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sthaug@nethelp.no wrote:
>> http://tservice.net.ru/~s0mbre/blog//devel/networking/dns/2008_08_08
>>
>> "Attack took about half of the day, i.e. a bit less than 10 hours.
>>  So, if you have a GigE lan, any trojaned machine can poison your DNS =
during
>>  one night... "
>>
>> Congratulations are due to Evgeniy Polyakov! He includes the source of=
 his
>> exploit.
>=20
> Interesting enough. Meanwhile, if I have a recursive name server where
> the total traffic from the authoritative servers is in the range of
> 2 - 3 Mbps, I believe I could safely rate limit the traffic from each
> individual IP (representing a possibly spoofed authoritative server) to=

> 100 - 200 kbps. This should raise the bar somewhat.

/me reconfigures the 1M-node botnets to only send 100 packets/s per bot.

Isn't distributed^Wcloud computing amazing?

Unfortunately, as long as one can try all the combinations in one way or =

another the problem keeps on existing. And if people can send 1G for 12=20
hours without nobody noticing, you have worse problems in your network.

Bad part is that one can most likely also crack dnssec or tls in this=20
method, it basically is the infinite monkeys typing problem, they will=20
produce the answer that you expected. If you work against it, eg "the=20
monkeys send me X fake responses lets ratelimit" you might be blocking=20
service (denial of service) to something legit again.

Nice and annoying problem, thanks Dan* :)

Greets,
  Jeroen

* =3D do the dictionaries already contain a proper definition for "to pul=
l=20
a Kaminsky on someone"? :)


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From owner-namedroppers@ops.ietf.org  Fri Aug  8 05:40:59 2008
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To: namedroppers@ops.ietf.org
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	Can someone fix majordomo to properly recognise base64
	encoded content.  Hint whitespace can occur *anywhere* in
	the base64 encoded content not just after a multiple of 4
	base64 characters.

	Mark

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From owner-namedroppers@ops.ietf.org  Fri Aug  8 05:41:26 2008
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To: namedroppers@ops.ietf.org
From: =?iso-8859-1?Q?=D3lafur?= =?iso-8859-1?Q?_Gu=F0mundsson?= /DNSEXT 
 chair <ogud@ogud.com>
Subject: DNSEXT/namedroppers list policy 
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Periodic posting, updated 08/Aug/2008. (new note well statement)

List Purpose:

   namedroppers at ops.ietf.org is the mailing list for the IETF DNSEXT
   (DNS EXTensions) working group.

   See <http://www.ietf.org/html.charters/dnsext-charter.html> for the
   WG charter.  Messages should be on topics appropriate to the DNSEXT
   WG, which are various discussion of the DNS protocols or
   administrivia of the WG itself.

- Specific items that are not appropriate for posting

   Calls for papers, announcements of events not directly relevant to
   the DNS protocols, etc. are not appropriate.

   Discussion of problems with particular implementations,
   announcements of releases, sites' misconfiguration, pleas for help
   with specific implementations, etc.  should be done on mailing lists
   for the particular implementations.

   There is a working group for DNS operational practice, DNSOP, whose
   charter can be found at
   <http://www.ietf.org/html.charters/dnsop-charter.html>. Items
   relevant to the DNSOP charter are to be discussed on the DNSOP
   mailing list.

   Discussion about the quality of implementations is outside the scope
   of this list.

Moderation:

   Moderator: DNSEXT chair(s) unless otherwise announced on mailing list.

   Moderation is based on "subscriber-only with spam filter". To
   counter a certain class of spam mails, messages over 20000
   characters, originating from list subscribers, will be held for
   moderations.

   Questions or concerns related to the acceptance or rejection of
   specific messages to the namedroppers mailing list should first be
   discussed with the WG chair, with follow up appeals using the normal
   appeals process of RFC 2026 (i.e. follow up with area directors, then
   IESG, etc.).


---

NOTE WELL:

Any submission to the IETF intended by the Contributor for 
publication as all or part of an IETF Internet-Draft or RFC and any 
statement made within the context of an IETF activity is considered 
an "IETF Contribution". Such statements include oral statements in 
IETF sessions, as well as written and electronic communications made 
at any time or place, which are addressed to:
the IETF plenary session,
any IETF working group or portion thereof,
the IESG, or any member thereof on behalf of the IESG,
the IAB or any member thereof on behalf of the IAB,
any IETF mailing list, including the IETF list itself, any working 
group or design team list, or any other list functioning under IETF auspices,
the RFC Editor or the Internet-Drafts function

All IETF Contributions are subject to the rules of RFC 3978 (updated 
by RFC 4748) and RFC 3979(updated by RFC 4879).

Statements made outside of an IETF session, mailing list or other 
function, that are clearly not intended to be input to an IETF 
activity, group or function, are not IETF Contributions in the 
context of this notice.

Please consult RFC 3978 (and RFC 4748) for details.

A participant in any IETF activity is deemed to accept all IETF rules 
of process, as documented in Best Current Practices RFCs and IESG Statements.

A participant in any IETF activity acknowledges that written, audio 
and video records of meetings may be made and may be available to the public.


IETF Secretariat - Please send problem reports to ietf-web@ietf.org. 


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From owner-namedroppers@ops.ietf.org  Fri Aug  8 05:42:58 2008
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From owner-namedroppers@ops.ietf.org  Fri Aug  8 06:05:56 2008
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Date: Fri, 8 Aug 2008 08:55:59 -0400
From: Andrew Sullivan <ajs@commandprompt.com>
To: namedroppers@ops.ietf.org
Subject: Please stop this thread (was: OFFTOPIC: DNSSEC groupthink versus
	improving DNS)
Message-ID: <20080808125558.GA56310@commandprompt.com>
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Dear colleagues,

Speaking as the one who has the current moderation token on this list,
I'd like to ask that we stop this thread.

Irrespective of what you personally think about DNSSEC, the liklihood
of its future deployment, its utility, the chances of it solving the
problems we have in the DNS, &c., the fact is that the WG adopted it,
and the specification is available.  Proposals for clarification,
discussion of what additional tools are needed (to the extent those
require protocol work), and even opposition to continued work in this
area are all on-topic for this working group.  Claims that DNSSEC will
never be deployed or that it is currently unworkable are _not_ on
topic here, because those claims have nothing to do with the protocol
itself.

Moreover, arguments that individuals are suffering from group-think
runs perilously close to the line of _ad hominem_ attack.  We have had
problems with that sort of discussion in the past, and I want to
remind everyone that we will not tolerate such attacks.  If you have a
problem with the protocol, feel free to discuss it here.  If you
instead have a problem just with what other people believe, then this
is not the right forum for your discussion.

Best regards,

Andrew

-- 
Andrew Sullivan
ajs@commandprompt.com
+1 503 667 4564 x104
http://www.commandprompt.com/

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Subject: Re: first succesful (lab) spoof of a fully source port randomized
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Ond=C5=99ej Sur=C3=BD wrote:
>> /me reconfigures the 1M-node botnets to only send 100 packets/s per bo=
t.
>=20
> Hmm, and how do you spoof source IP address together with not being blo=
cked by
> per source IP limit filter?

Why bother with spoofing? You have a million *real* hosts available, and =

soon, because of DNS hijacking and then $tricks quite a number more.

We really have to be happy that the updates provided by at least Windows =

Update are reasonably secure ;)

Greets,
  Jeroen


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From owner-namedroppers@ops.ietf.org  Fri Aug  8 07:09:13 2008
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Paul Vixie wrote:
>
>   which is not to say
> that dnssec is easy -- i know that at ISC we're thinking seriously of
> dedicating the whole BIND 9.7 release to dnssec tools and usability.

This is a good idea.

We really need a single checkbox "Automatically sign all my zones" in the 
nameserver implementations.

That, and not the protocol itself is holding up DNSSEC deployment. IMHO and 
all that.

But back to the namedropper charter:

  * Are there any open protocol issues which make such a "single checkbox"
    deployment of DNSSEC impossible?

  * In order to facilitate this, we need automatic DS generation in the
    parent zone, and means to deal with lost keys and other
    "crypto-emergencies". Is this all defined?

What I really want is a Debian upgrade which just asks for my confirmation 
to enable DNSSEC on my box without any further interactions.

/ol
-- 
// Otmar Lendl <lendl@nic.at>, T: +43 1 5056416 - 33, F: - 933 //

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From: bmanning@vacation.karoshi.com
To: Duane at e164 dot org <duane@e164.org>
Cc: David Ulevitch <davidu@everydns.net>,
   Namedroppers <namedroppers@ops.ietf.org>
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 "Duane" - David is not the only one... he's just more vocal.
 you invite confusion ...  

 based on public records, I will presume this is you until or unless
 othewise proven by credible parties.

Duane Groth
P.O. Box 75
Banksia
NSW 2216 AU

--bill



On Fri, Aug 08, 2008 at 04:37:22PM +1000, Duane at e164 dot org wrote:
> David Ulevitch wrote:
> > Duane,
> > 
> > Can we get a last name please? We already have one Duane on this list
> > and it's hard to know who you are.  Is that too much to ask?  This is an
> > IETF mailing list, after all.
> 
> In all the time I've used the internet you are the only person to care
> at all.
> 
> -- 
> 
> Best regards,
>  Duane
> 
> --
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From owner-namedroppers@ops.ietf.org  Fri Aug  8 16:42:50 2008
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Date: Fri, 8 Aug 2008 19:37:51 -0400
From: Matt Larson <mlarson@verisign.com>
To: namedroppers@ops.ietf.org
Subject: Re: Please stop this thread (was: OFFTOPIC: DNSSEC groupthink versus improving DNS)
Message-ID: <20080808233750.GA1799@sirocco.local>
References: <489AD5E3.20708@nlnetlabs.nl> <20080807134236.GA19024@outpost.ds9a.nl> <F153E1C5-6E05-475A-897D-471398D161C9@NLnetLabs.nl> <20080808125558.GA56310@commandprompt.com>
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On Fri, 08 Aug 2008, Andrew Sullivan wrote:
> Moreover, arguments that individuals are suffering from group-think
> runs perilously close to the line of _ad hominem_ attack.  We have had
> problems with that sort of discussion in the past, and I want to
> remind everyone that we will not tolerate such attacks.  If you have a
> problem with the protocol, feel free to discuss it here.  If you
> instead have a problem just with what other people believe, then this
> is not the right forum for your discussion.

I wasn't going to jump into this thread, but I can't let this message
pass without comment.

Your message prompted me to re-read Bert's original "group-think"
message and I find nothing inappropriate about it.  It was certainly
not "perilously close to the line of _ad hominem_ attack", nor was it
an attack at all.  I'd argue it was even on-topic, in that it
questions if we're all doing the best engineering we can.

How big is the worldwide DNS protocol engineering community?
Certainly no more than hundreds of people.  We have been breathing our
own DNSSEC exhaust fumes for a long time.  Personally, I find it
refreshing for someone with demonstrated clue to come in and politely
question things.

I've seen several creative proposals to deal with the recently
described cache-poisoning attacks and the urgency will spur further
creative thinking.  A hop-by-hop solution of adding more entropy would
go a long way to addressing this attack.  The lack of will I have
perceived recently in this working group to pursue non-DNSSEC
solutions frustrates me.  A lot of us have a lot invested in DNSSEC,
but shame on us as engineers if this is the only hammer in our toolbox
and we use it to hit every nail.

So I join Bert in asking everyone to keep an open mind, think
critically and keep engineering.

Matt

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From owner-namedroppers@ops.ietf.org  Fri Aug  8 17:18:22 2008
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bmanning@vacation.karoshi.com wrote:
>  "Duane" - David is not the only one... he's just more vocal.
>  you invite confusion ...  

Basing identity on names is pointless, especially with how easily mail
headers can be spoofed, well not even spoofed, but 'set'.

Although should there be an uproar about you not setting your full name?

>  based on public records, I will presume this is you until or unless
>  othewise proven by credible parties.

You can presume what ever you wish, does it change who I am by what name
I choose to be known as?

I wonder how the guy went who allegedly changed his name legally to Sony
Playstation...

http://www.wattpad.com/72957-List-of-unusual-personal-names-

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Fri Aug  8 18:14:04 2008
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Subject: Re: Please stop this thread (was: OFFTOPIC: DNSSEC groupthink versus improving DNS)
Date: Fri, 8 Aug 2008 18:07:51 -0700
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Matt,

> Your message prompted me to re-read Bert's original "group-think"
> message and I find nothing inappropriate about it.  It was certainly
> not "perilously close to the line of _ad hominem_ attack", nor was it
> an attack at all.  I'd argue it was even on-topic, in that it
> questions if we're all doing the best engineering we can.

There is a difference between questioning whether we're doing the best  
that we can and implicitly accusing some number of us of intellectual  
laziness (at best) or actual dishonesty (at worst).

As you may be aware, I am no fan of DNSSEC (to put it mildly) and have  
actively argued caution on spending resources on deploying DNSSEC in  
numerous venues because I felt the cost outweighed the benefits it  
would bring towards ameliorating the risks inherent in the DNS and  
felt those resources would be better applied to things like routing  
security.  I have since changed my mind.  The cost of deploying DNSSEC  
is high, however the risk is greater than I originally estimated,  
hence I believe the benefit is worth the cost.  I still feel  
significant work needs to be done to DNSSEC to make it an effective  
defense, but it is clear to me that it is the right direction to go  
and we should go that direction sooner rather than later.

Others may feel differently.  However, I would not label those  
individuals nor would I accuse them of engaging in some deprecatory  
psychobabble buzzword of the day.  Such labeling and accusations  
needlessly polarize discussions, which I feel does not contribute  
towards forward motion.

But maybe that's just me.

> A hop-by-hop solution of adding more entropy would
> go a long way to addressing this attack.

This particular instantiation of the attack, maybe (how do you protect  
against on-the-datapath spoofing with hop-by-hop entropy addition?).   
However, again, it is treating the symptoms, not the disease.  How  
many times does the DNS community have to be bitten by the same  
fundamental bug before we finally squash that bug?  Do you or Bert or  
any of his <aol>Me too!</aol> supporters think the problem is going to  
get better over time with computers (and hence zombies) and networks  
constantly getting better/faster/more numerous?

> The lack of will I have
> perceived recently in this working group to pursue non-DNSSEC
> solutions frustrates me.

I'm sorry, what lack of will are you talking about?  I seem to recall  
a number of drafts being proposed and discussed that are not DNSSEC- 
related.  Forgery-resilience and dns-0x20 are two examples.  I have  
seen numerous people ask for solutions other than DNSSEC that address  
the fundamental weakness in the DNS. I myself would love to see an  
alternative to the bloated pig of a protocol, yet most of what I have  
seen appears to add even more fragility than DNSSEC and/or doesn't  
address the fundamental problem.

> So I join Bert in asking everyone to keep an open mind, think
>>
> critically and keep engineering.

Suggestions of keeping an open mind and thinking critically should  
also be applied to those who do not want to implement DNSSEC (for  
whatever reason).

Regards,
-drc



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From owner-namedroppers@ops.ietf.org  Sat Aug  9 19:15:35 2008
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Duane wrote:
> Mark Andrews wrote:
> 
>> 	Well we could stop caching any DNS data.  That's the only
>> 	way to make it match the credit card industry model where
>> 	changes are instantly available.
> 
> Anyone have any idea how many credit card transactions per second occur?

Far fewer than domain lookups.

-- 
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"There is no limit to what a man can do or how far he can go if he
doesn't mind who gets the credit." - Robert Woodruff

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From owner-namedroppers@ops.ietf.org  Sat Aug  9 21:29:51 2008
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From: bmanning@vacation.karoshi.com
To: Ben Laurie <ben@links.org>
Cc: Namedroppers <namedroppers@ops.ietf.org>
Subject: how many angels can dance on the head of a pin?
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On Sun, Aug 10, 2008 at 03:07:00AM +0100, Ben Laurie wrote:
> >Mark Andrews wrote:
> >
> >>	Well we could stop caching any DNS data.  That's the only
> >>	way to make it match the credit card industry model where
> >>	changes are instantly available.


	these days, i am thinking Mark is just baiting trolls.
	caches are too useful to abandon outright, but i'm pretty sure
	rethinking them is a great idea.


--bill

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Subject: Re: how many angels can dance on the head of a pin?
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bmanning@vacation.karoshi.com wrote:
> On Sun, Aug 10, 2008 at 03:07:00AM +0100, Ben Laurie wrote:
>>> Mark Andrews wrote:
>>>
>>>> 	Well we could stop caching any DNS data.  That's the only
>>>> 	way to make it match the credit card industry model where
>>>> 	changes are instantly available.
> 
> 
> 	these days, i am thinking Mark is just baiting trolls.
> 	caches are too useful to abandon outright, but i'm pretty sure
> 	rethinking them is a great idea.

Caches seem to be the majority of concern in the last 3 to 4 weeks, I
doubt anyone would disagree they can be useful just like web caching can
be useful.

The question is does the pros outweigh the cons?

If shared caching at the ISP level is abandoned in favour of moving them
closer to the end user, either on their computer or on the LAN but isn't
accessible usually from beyond the LAN, would that not solve the
majority of concerns currently being expressed?

-- 

Best regards,
 Duane

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To: jeroen@unfix.org
Cc: namedroppers@ops.ietf.org
Subject: Re: first succesful (lab) spoof of a fully source port randomized
 server reported
From: sthaug@nethelp.no
In-Reply-To: <489C324B.1090603@spaghetti.zurich.ibm.com>
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> > Interesting enough. Meanwhile, if I have a recursive name server where
> > the total traffic from the authoritative servers is in the range of
> > 2 - 3 Mbps, I believe I could safely rate limit the traffic from each
> > individual IP (representing a possibly spoofed authoritative server) to
> > 100 - 200 kbps. This should raise the bar somewhat.
> 
> /me reconfigures the 1M-node botnets to only send 100 packets/s per bot.
> 
> Isn't distributed^Wcloud computing amazing?

The attacker needs to spoof a *specific* source IP. The 1M node botnet
doesn't help here. As Paul Vixie said on bind-users today:

> note that any dns server with a host based firewall can implement a 100%
> effective mitigation for the Polyakov attack, and it's possible that an
> upstream/outboard firewall could also be made to do it.  in freebsd ipfw
> it looks like this:
> 
> add     pipe 1  udp     from any 53 to 204.152.188.20 in
> pipe 1  config  mask src-ip 0xffffffff buckets 32768 bw 56Kbit/s queue 1

which is exactly what I was thinking of.

Steinar Haug, Nethelp consulting, sthaug@nethelp.no

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From owner-namedroppers@ops.ietf.org  Sun Aug 10 01:53:04 2008
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Date: Sun, 10 Aug 2008 09:50:35 +0100
From: Alex Bligh <alex@alex.org.uk>
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To: Duane at e164 dot org <duane@e164.org>, bmanning@vacation.karoshi.com,
 Namedroppers <namedroppers@ops.ietf.org>
cc: Alex Bligh <alex@alex.org.uk>
Subject: Re: how many angels can dance on the head of a pin?
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--On 10 August 2008 16:24:54 +1000 Duane at e164 dot org <duane@e164.org> 
wrote:

> If shared caching at the ISP level is abandoned in favour of moving them
> closer to the end user, either on their computer or on the LAN but isn't
> accessible usually from beyond the LAN, would that not solve the
> majority of concerns currently being expressed?

I think ISP-level caching has only been targeted here because it's the most
obvious way to obtain maximum impact for a cache poisoning attack. However,
unfortunately, it's not the only way to use cache poisoning techniques.
Not using ISP-level caching means (aside from the increased load):

  1. Lookups would more often take place from behind a NAT. This can reduce
     entropy and make any given attack easier. Thus remember unlike many
     attack profiles, sticking a shared cache behind a NAT only serves
     to make things worse.

  2. For specifically targeted attacks (e.g. where what Mallory really
     wants to do is poison the DNS for a particular mail smarthost), it
     gets no more difficult.

Let's also remember that no intermediate caching at all means lots
of additional load and complexity on the end user device (as full caching
and recursion needs to be implemented there) and/or greater latency,
as the recursive element requires lookups from "." upwards go over
an end user link. Consider how, for instance, internet browsing on a mobile
phone would be affected by a total absence of intermediate caching servers.

To return to the original angels and pins discussion, when this group
was first busying itself designing just how the lipstick might be applied
to the DNSSEC pig, one of the original design criteria was that the security
worked in such a way that it was transparent to dumb caches between
authoritative server and end resolver. Solving integrity problems without
dumb caches being the ones providing the data (i.e. assuming resolver
could always talk directly to the authoritative server) would have been
far easier, and would no doubt have resulted in a far less ugly beast
of a protocol. If we were wrong to include caching as a design criterion
at all (i.e. if we can ditch it now), then yes, that is seems consistent
with your view of DNSSEC. I don't, however, think dropping caching is
a realistic option, either for vanilla DNS or for DNSSEC or any substitute
thereof.

Alex

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From owner-namedroppers@ops.ietf.org  Sun Aug 10 01:54:59 2008
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From: Alex Bligh <alex@alex.org.uk>
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To: sthaug@nethelp.no, jeroen@unfix.org
cc: namedroppers@ops.ietf.org, Alex Bligh <alex@alex.org.uk>
Subject: Re: first succesful (lab) spoof of a fully source port randomized
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--On 10 August 2008 09:37:18 +0200 sthaug@nethelp.no wrote:

> The attacker needs to spoof a *specific* source IP. The 1M node botnet
> doesn't help here. As Paul Vixie said on bind-users today:

Let's suppose the attacker /does/ spoof a specific source IP (or a small
group thereof), and uses it to target servers configured like this...

>> note that any dns server with a host based firewall can implement a 100%
>> effective mitigation for the Polyakov attack, and it's possible that an
>> upstream/outboard firewall could also be made to do it.  in freebsd ipfw
>> it looks like this:
>>
>> add     pipe 1  udp     from any 53 to 204.152.188.20 in
>> pipe 1  config  mask src-ip 0xffffffff buckets 32768 bw 56Kbit/s queue 1
>
> which is exactly what I was thinking of.

...I think we've just succeeded in converting a poisoning attack into
a DoS vector. Just spoof the IPs of the root nameservers, or NS for
google.com or whatever. I realise DoS of root nameserver access is probably
less dangerous that poisoning then, but...

Alex

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Subject: Re: how many angels can dance on the head of a pin?
References: <200808080237.m782bBqk005628@drugs.dv.isc.org> <489BBA1C.1040107@e164.org> <489E4D44.1080306@links.org> <20080810042136.GA18568@vacation.karoshi.com.> <489E89B6.6090208@e164.org> <01B9CF1DF0A4A4443A6E73A4@nimrod.local>
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Alex Bligh wrote:

>  1. Lookups would more often take place from behind a NAT. This can reduce
>     entropy and make any given attack easier. Thus remember unlike many
>     attack profiles, sticking a shared cache behind a NAT only serves
>     to make things worse.

I fail to see how this would apply, the reason for randomising the ports
was for publicly accessible caches, such that ISPs run, which can be
queried by the attacker and also for the attacker to send fake replies
at the same time.

If the attacker can't send requests and replies they would need to be in
the path to alter things.

-- 

Best regards,
 Duane

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Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
References: <200808080052.m780qMd2002912@drugs.dv.isc.org>
Date: Sun, 10 Aug 2008 11:16:57 +0200
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	message of "Fri, 08 Aug 2008 10:52:22 +1000")
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* Mark Andrews:

> 	You could have online keys and sign every response with a
> 	ttl + clock skew based window.  This requires that the
> 	private key is on all slaves.  The crypto hardware guys
> 	will love you :-)

Crypto accelerators for RSA are dead.  You can buy four 64x64 -> 128 bit
multipliers supporting a rate of more than 0.5 billion multiplications
per second each for 150 EUR.

> 	Which can be completely automated.  Has already been in
> 	some senarios.  I havn't re-signed my zones for months
> 	despite using a 30 day expiry period on the signatures.
>
> 	It is set and forget.  More and more of the process will
> 	become "set and forget" as the tools develop.

It's not just the tools.  It requires a change of minds, too.  For a
long time, DNSSEC operations were based not on classic DNS approaches,
but on the CA/PKI model (involving off-line keys, different registration
requirements, audit trails etc.).  However, for obvious reasons, hardly
anybody wanted to deploy it this way.

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From owner-namedroppers@ops.ietf.org  Sun Aug 10 02:23:00 2008
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Date: Sun, 10 Aug 2008 10:22:27 +0100
From: Alex Bligh <alex@alex.org.uk>
Reply-To: Alex Bligh <alex@alex.org.uk>
To: Duane at e164 dot org <duane@e164.org>
cc: bmanning@vacation.karoshi.com, Namedroppers <namedroppers@ops.ietf.org>,
 Alex Bligh <alex@alex.org.uk>
Subject: Re: how many angels can dance on the head of a pin?
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References: <200808080237.m782bBqk005628@drugs.dv.isc.org>
 <489BBA1C.1040107@e164.org> <489E4D44.1080306@links.org>
 <20080810042136.GA18568@vacation.karoshi.com.> <489E89B6.6090208@e164.org>
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--On 10 August 2008 19:07:25 +1000 Duane at e164 dot org <duane@e164.org> 
wrote:

>>  1. Lookups would more often take place from behind a NAT. This can
>>  reduce entropy and make any given attack easier. Thus remember unlike
>>     many attack profiles, sticking a shared cache behind a NAT only
>>     serves to make things worse.
>
> I fail to see how this would apply, the reason for randomising the ports
> was for publicly accessible caches, such that ISPs run, which can be
> queried by the attacker and also for the attacker to send fake replies
> at the same time.
>
> If the attacker can't send requests and replies they would need to be in
> the path to alter things.

Some NATs (e.g.) have the behaviour of using a constant source port by
DNS, or a source port incrementing by 1 for each query (which is just
as bad). So, if the caching resolver is behind that NAT (or more
accurately NAPT) then simply spoof the NAT's external IP address and
guess the source port it used (using that as your destination port).
The NAT then helpfully rewrites this to the randomised source port
inside the NAT. Roy Arends has been doing a survey of NAT behaviour.
I'm not sure whether he's demonstrated poisoning through broken NAT
with a randomised source port cache in the lab, but I don't think it
should be hard; a NAPT which rewrites the source port to a constant
value effectively removes all the entropy given by the recent bind
patches. I mentioned this on namedroppers a while ago but I
was being somewhat cryptic as the nature of the attack itself wasn't
public then.

Alex

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From owner-namedroppers@ops.ietf.org  Sun Aug 10 02:33:44 2008
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Date: Sun, 10 Aug 2008 10:31:41 +0100
From: Alex Bligh <alex@alex.org.uk>
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To: Alex Bligh <alex@alex.org.uk>, Duane at e164 dot org <duane@e164.org>
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--On 10 August 2008 10:22:27 +0100 Alex Bligh <alex@alex.org.uk> wrote:

> Some NATs (e.g.) have the behaviour of using a constant source port by
> DNS, or a source port incrementing by 1 for each query (which is just
> as bad).

I should have added that whilst non-broken NATs don't make things worse
(*), they also don't make things better.

* = though arguably anything that compresses the

> If the attacker can't send requests and replies they would need to be in
> the path to alter things.

The data path being directly attacked is that from the caching server
(via the NAT) to the authoritative server (which is partly outside the NAT)
not between the stub resolver and the caching server (which is entirely
inside the NAT).

Alex

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 namedroppers@ops.ietf.org
Subject: Re: how many angels can dance on the head of a pin?
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> >  1. Lookups would more often take place from behind a NAT. This can reduce
> >     entropy and make any given attack easier. Thus remember unlike many
> >     attack profiles, sticking a shared cache behind a NAT only serves
> >     to make things worse.
> 
> I fail to see how this would apply, the reason for randomising the ports
> was for publicly accessible caches, such that ISPs run, which can be
> queried by the attacker and also for the attacker to send fake replies
> at the same time.

At least for the ISP *I* work for, our publicly accessible caches are
accessible for direct recursive queries only from IP addresses within
our own AS, not from the Internet at large.

There are of course lots ways an attacker can *indirectly* get queries
to be made from IPs within our AS (see for instance Dan Kaminsky's
presentation). On the other hand, we implement RPF checking for our
customers, so an attacker can *not* easily get our customers to spoof
addresses and thus participate in the poisoning part of the attack.

Steinar Haug, Nethelp consulting, sthaug@nethelp.no

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References: <200808080237.m782bBqk005628@drugs.dv.isc.org> <489BBA1C.1040107@e164.org> <489E4D44.1080306@links.org> <20080810042136.GA18568@vacation.karoshi.com.> <489E89B6.6090208@e164.org> <01B9CF1DF0A4A4443A6E73A4@nimrod.local> <489EAFCD.2090204@e164.org> <6751CAB7406138E7F72B474E@nimrod.local> <70CC931622BD9710F13283EA@nimrod.local>
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Alex Bligh wrote:
> 
> 
> --On 10 August 2008 10:22:27 +0100 Alex Bligh <alex@alex.org.uk> wrote:
> 
>> Some NATs (e.g.) have the behaviour of using a constant source port by
>> DNS, or a source port incrementing by 1 for each query (which is just
>> as bad).
> 
> I should have added that whilst non-broken NATs don't make things worse
> (*), they also don't make things better.

Not so, actually. If the NAT does random port assignment, then the 
resolver's assignment can be predictable.

-- 
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doesn't mind who gets the credit." - Robert Woodruff

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From owner-namedroppers@ops.ietf.org  Sun Aug 10 05:06:15 2008
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Date: Sun, 10 Aug 2008 13:01:26 +0100
From: Alex Bligh <alex@alex.org.uk>
Reply-To: Alex Bligh <alex@alex.org.uk>
To: Ben Laurie <ben@links.org>
cc: Duane at e164 dot org <duane@e164.org>, bmanning@vacation.karoshi.com,
 Namedroppers <namedroppers@ops.ietf.org>, Alex Bligh <alex@alex.org.uk>
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References: <200808080237.m782bBqk005628@drugs.dv.isc.org>
 <489BBA1C.1040107@e164.org> <489E4D44.1080306@links.org>
 <20080810042136.GA18568@vacation.karoshi.com.> <489E89B6.6090208@e164.org>
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Ben,

--On 10 August 2008 12:30:10 +0100 Ben Laurie <ben@links.org> wrote:

>> I should have added that whilst non-broken NATs don't make things worse
>> (*), they also don't make things better.
>
> Not so, actually. If the NAT does random port assignment, then the
> resolver's assignment can be predictable.

Yep quite possibly. My post was precaffeinated and I was referring to
resolvers that were fixed-up, i.e. unpredictable. In practice though, I
suspect (Roy will know better) that a NAT seeing traffic from a single
internal (src IP, src port) tuple will continue to map that to a single
external (src IP, src port) tuple because, unless it's doing deeper
inspection than normal, it doesn't know which packets form separable
conversations. So the improvement would only occur where the broken
resolver used a non-constant but predictable port, which is the minority of
cases.

My point was that one should not think one can just stick a caching
resolver behind a NAT device and suddenly achieve immunity from this
particular poisoning attack. I presume you agree with that?

Alex

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To: Alex Bligh <alex@alex.org.uk>
CC: Duane at e164 dot org <duane@e164.org>, 
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Subject: Re: how many angels can dance on the head of a pin?
References: <200808080237.m782bBqk005628@drugs.dv.isc.org> <489BBA1C.1040107@e164.org> <489E4D44.1080306@links.org> <20080810042136.GA18568@vacation.karoshi.com.> <489E89B6.6090208@e164.org> <01B9CF1DF0A4A4443A6E73A4@nimrod.local> <489EAFCD.2090204@e164.org> <6751CAB7406138E7F72B474E@nimrod.local> <70CC931622BD9710F13283EA@nimrod.local> <489ED142.8010500@links.org> <9638F8EA548C822160EF40E4@nimrod.local>
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Alex Bligh wrote:
> Ben,
> 
> --On 10 August 2008 12:30:10 +0100 Ben Laurie <ben@links.org> wrote:
> 
>>> I should have added that whilst non-broken NATs don't make things worse
>>> (*), they also don't make things better.
>>
>> Not so, actually. If the NAT does random port assignment, then the
>> resolver's assignment can be predictable.
> 
> Yep quite possibly. My post was precaffeinated and I was referring to
> resolvers that were fixed-up, i.e. unpredictable. In practice though, I
> suspect (Roy will know better) that a NAT seeing traffic from a single
> internal (src IP, src port) tuple will continue to map that to a single
> external (src IP, src port) tuple because, unless it's doing deeper
> inspection than normal, it doesn't know which packets form separable
> conversations. So the improvement would only occur where the broken
> resolver used a non-constant but predictable port, which is the minority of
> cases.
> 
> My point was that one should not think one can just stick a caching
> resolver behind a NAT device and suddenly achieve immunity from this
> particular poisoning attack. I presume you agree with that?

Depends on your resolver, as you explained above.

-- 
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doesn't mind who gets the credit." - Robert Woodruff

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From owner-namedroppers@ops.ietf.org  Sun Aug 10 08:46:58 2008
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From: Paul Vixie <vixie@isc.org>
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             <20080810.130723.71154003.sthaug@nethelp.no> 
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> From: sthaug@nethelp.no
> 
> At least for the ISP *I* work for, our publicly accessible caches are
> accessible for direct recursive queries only from IP addresses within
> our own AS, not from the Internet at large.

may i ask that you write an FYI RFC for dnsop explaining this policy with
special emphasis on (1) how you did it, (2) how easy it was to do it, and
(3) how beneficial it's been that you did it.  many of your coopetitors
across the industry are not yet following in these excellent footsteps.

(and it won't make you safe from spoofing if you have a dialup or enduser
population who can be infested with bots, or if you have SMTP servers who
can be triggered to make DNS requests for an attacker with very fine
timing, but this kind of network hygiene certainly limits the scope of
the problem.)

(if you also enforce BCP38 against your customers, you might mention this
in passing in your FYI RFC, again explaining how easy it was and how much
cost and/or benefit you get from it.)

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From owner-namedroppers@ops.ietf.org  Sun Aug 10 08:47:02 2008
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References: <200808080237.m782bBqk005628@drugs.dv.isc.org>
 <489BBA1C.1040107@e164.org> <489E4D44.1080306@links.org>
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Date: Sun, 10 Aug 2008 08:38:41 -0700
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Subject: Re: how many angels can dance on the head of a pin?
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"Caching" is not the currently-discussed problem: it is a too-brief 
shorthand for the currently-discussed problem.

A better problem statement might be "caches (a) that can be easily 
poisoned and (b) from which data that will be trusted by compliant 
resolvers will be served". This WG seems to be trying to make (a) 
harder to make the attack harder.

We haven't spent much time analyzing how to fix (b), which might give 
us a much better fix. Assuming a poisoned cache, if either the poison 
is never emitted from the cache, or if resolvers stop believing 
emitted poison, the attack fails completely.

--Paul Hoffman, Director
--VPN Consortium

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From owner-namedroppers@ops.ietf.org  Sun Aug 10 11:09:26 2008
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Subject: RE: How do we get the whole world to upgrade to DNSSEC capable resolvers?
Date: Sun, 10 Aug 2008 20:02:06 +0200
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Danny Mayer wrote:
> > I agree - and I am not arguing against DNSSEC as a whole.
> > As I started out saying - "There may be other good reasons to push
> DNSSEC" - distributing public keys certainly may be one of those.
> > However, this was in regards to the Kaminsky bug, which is all about
> carrying IP addresses (A/AAAA RRSets in response Additional section).
> > So to clarify: DNSSEC doesn't make much difference when the bad guy
> > is on-the-wire - for IP address records.
> That's not true either way. DNSSEC will protect you from the bad guy on
> the wire.

My point was that it doesn't matter that you get the correct IP address
(signed by DNSSEC) if the bad buy is on the wire.
In that scenario he can just spoof that IP address and replace web-sites
etc. with his own data.
Only SSL can protect you here.


> But the A/AAAA records in the additional section is not the
> only part that needs protection. The authority section also needs
> protection since they contain the authorative nameserver names. By
> diverting further queries to their own nameservers they no longer need
> a cachepoisoning attack.

Right - but NS-records point to host names which point to A/AAAA records
which point to IP addresses.
Comes back to the same thing - if the bad guy is on the wire, you are still
in trouble...
DNSSEC or not.


> > Without having thought this through, I think resolvers could probably
> > ignore anything else (non A/AAAA RRSets) in the response Additional
> section - limiting the Kaminsky bug to such records. But that's a
> different thread... 
> And what about the authority section?

Se above.


> > Carrying IP addresses is still by far the biggest use of DNS.
> No it isn't. MX records are almost as big. And then there are SRV
> records.

OK - but MX-records point to host names which point to A/AAAA records which
point to IP addresses...
If the bad guy is on the wire, he can intercept and replace your SMTP
traffic anyway. 
DNSSEC or not.

SRV-records also point to host names which...


> > And I am just not convinced that it is a good idea to apply DNSSEC's
> complexity to this most fundamental part of our Internet.
> > I believe a simpler solution stands a much better chance of actually
> being implemented and used, and therefore is more secure overall.
> > Especially if such a solution does not require any end-user action
> other than patching.
> Go look at Dan Kaminsky's slides for the fuller picture

I see nothing in the slides that suggest that DNSSEC is the only true
solution or that rule out other solutions.
On the contrary it seems to me that Dan Kaminsky himself is suggesting other
solutions in his latest blog entry on the matter...


Sincerely,
Jesper



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From owner-namedroppers@ops.ietf.org  Sun Aug 10 11:37:06 2008
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             <1BDC660168661516D7087994@nimrod.local> 
References: <20080808111242.GI6566@outpost.ds9a.nl> <20080808.132607.41660169.sthaug@nethelp.no> <489C324B.1090603@spaghetti.zurich.ibm.com> <20080810.093718.74690983.sthaug@nethelp.no>  <1BDC660168661516D7087994@nimrod.local> 
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> >> add     pipe 1  udp     from any 53 to 204.152.188.20 in
> >> pipe 1  config  mask src-ip 0xffffffff buckets 32768 bw 56Kbit/s queue 1

> ...I think we've just succeeded in converting a poisoning attack into a
> DoS vector. Just spoof the IPs of the root nameservers, or NS for
> google.com or whatever. I realise DoS of root nameserver access is
> probably less dangerous that poisoning then, but...

there are easier ways to DoS a nameserver.  this isn't an exciting new vector.

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From owner-namedroppers@ops.ietf.org  Mon Aug 11 09:39:33 2008
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From: bmanning@vacation.karoshi.com
To: Duane at e164 dot org <duane@e164.org>
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> >>>> 	Well we could stop caching any DNS data.  That's the only
> >>>> 	way to make it match the credit card industry model where
> >>>> 	changes are instantly available.
> > 
> > 
> > 	these days, i am thinking Mark is just baiting trolls.
> > 	caches are too useful to abandon outright, but i'm pretty sure
> > 	rethinking them is a great idea.
> 
> Caches seem to be the majority of concern in the last 3 to 4 weeks, I
> doubt anyone would disagree they can be useful just like web caching can
> be useful.
> 
> The question is does the pros outweigh the cons?
> 
> If shared caching at the ISP level is abandoned in favour of moving them
> closer to the end user, either on their computer or on the LAN but isn't
> accessible usually from beyond the LAN, would that not solve the
> majority of concerns currently being expressed?
> 
> -- 
> 
> Best regards,
>  Duane


	if your caching at all (near/far) your caching.
	if you keep zero state "...stop caching any DNS data... (Mark Andrews)"
	then you are not.

	my gentle assertion was that caching is valuable, should be kept/rethought.
	theevents of the day are only tangential to cache design.  -IF- caching is
	to be re-thought, then it should be carefully thought out, not a twitch
	reaction to a (perceived) threat.


--bill

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To: namedroppers@ops.ietf.org
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers? 
In-reply-to: Your message of "Sun, 10 Aug 2008 20:02:06 +0200."
             <021101c8fb13$34634310$9d29c930$@com> 
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> OK - but MX-records point to host names which point to A/AAAA records which
> point to IP addresses...
> If the bad guy is on the wire, he can intercept and replace your SMTP
> traffic anyway. 
> DNSSEC or not.
> 
> SRV-records also point to host names which...

	DNS security is required for SMTP security to work.  How
	else fo you securely workout who you are supposed to be
	communicating with.

	Mark
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Mon Aug 11 12:12:32 2008
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From: "Jay R. Ashworth" <jra@baylink.com>
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Subject: Why *can* cached DNS replies be overwritten?
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[ cross-posted from NANOG, cause vix told me to :-)

On Mon, Aug 11, 2008 at 11:20:07AM -0400, Leo Bicknell wrote:
> If your vendor told you that you are not at risk they are wrong,
> and need to go re-read the Kaminski paper.  EVERYONE is vunerable,
> the only question is if the attack takes 1 second, 1 minute, 1 hour
> or 1 day.  While possibly interesting for short term problem
> management none of those are long term fixes.  I'm not sure your
> customers care when .COM is poisoned if it took the attacker 1
> second or 1 day.

Correct me if I'm wrong, Leo, but your assertion turns on the fact that
the server will accept an overwriting cache entry for something it
already has cacheed, does it not?

Do djb and Power in fact do that?

If they don't, the window of opportunity to poison something like .com
is limited to the period between when that entry expires from the local
server's cache and the next time it hears a reply -- which will be the
time after that expiry when someone next requests a .com name; IE
almost immediately, no?

Everyone seems to continue asking "why can poisoning overwrite already
cached answer" and no one seems to be answering, and, unless I'm a
moron (which is not impossible), that's the crux of this issue.

Cheers,
-- jra
-- 
Jay R. Ashworth                   Baylink                      jra@baylink.com
Designer                     The Things I Think                       RFC 2100
Ashworth & Associates     http://baylink.pitas.com                     '87 e24
St Petersburg FL USA      http://photo.imageinc.us             +1 727 647 1274

	     Those who cast the vote decide nothing.
	     Those who count the vote decide everything.
	       -- (Josef Stalin)


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From owner-namedroppers@ops.ietf.org  Mon Aug 11 13:08:34 2008
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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers?
Date: Mon, 11 Aug 2008 13:04:07 -0700
References: <48875934.8080101@links.org> <F113C53F-D189-45A0-8DC3-14725395D1BD@virtualized.org> <20080723183227.GA11957@outpost.ds9a.nl> <028601c8f185$eeb51b90$cc1f52b0$@com> <F64EF155F05968A001280C7B@Ximines.local> <028a01c8f18c$7f6bb620$7e432260$@com> <572015C3F44995F54736D38B@Ximines.local> <029401c8f196$c5822bd0$50868370$@com> <489F0F8E.6020607@gis.net> <021101c8fb13$34634310$9d29c930$@com>
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Jesper,

On Aug 10, 2008, at 11:02 AM, Jesper G. H=F8y wrote:
> My point was that it doesn't matter that you get the correct IP =20
> address
> (signed by DNSSEC) if the bad buy is on the wire.

> In that scenario he can just spoof that IP address and replace web-=20
> sites etc. with his own data.


Ignoring for the moment the fact that 134 million (or even 4 billion) =20=

packets isn't that much anymore (and will be less and less over time), =20=

the DNS lookup 'wire' is logically distinct from the content 'wire'.  =20=

The ability to "intercept spoof" a DNS response can occur anywhere on =20=

the DNS lookup 'wire', not only on the content producer/consumer's =20
local LAN.  By not protecting the packet content, you open yourself up =20=

to a distinct set of attackers beyond the local wire.

> Only SSL can protect you here.

As Dan Kaminsky points out: "SSL certs themselves are dependent on the =20=

DNS".

> I see nothing in the slides that suggest that DNSSEC is the only true
> solution or that rule out other solutions.

Indeed.  DNSSEC may not be the 'only true solution' and there may be =20
other solutions.  The vast majority of folks who have burned brain =20
cells and stomach lining on DNSSEC could be complete idiots and an =20
obvious, complete, lightweight, and architecturally clean solution =20
could be staring all of us in the face.  I look forward to reading =20
your draft on the topic  (note that I wouldn't consider a solution =20
that ignores the risk on the DNS lookup 'wire' complete, but maybe =20
that's just me).

I would however note that partly as a result of this latest incident =20
of having it pointed out that it is better to protect data content =20
than the data channel, the amount of DNS infrastructure out there =20
capable of supporting DNSSEC (and the political will to see it =20
deployed) has likely taken a very significant jump...

Regards,
-drc


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To: Mark Andrews <Mark_Andrews@isc.org>,namedroppers@ops.ietf.org
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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable
  resolvers? 
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At 09:18 PM 8/10/2008, Mark Andrews wrote:

>> OK - but MX-records point to host names which point to A/AAAA records which
>> point to IP addresses...
>> If the bad guy is on the wire, he can intercept and replace your SMTP
>> traffic anyway. 
>> DNSSEC or not.
>> 
>> SRV-records also point to host names which...
>
>        DNS security is required for SMTP security to work. 

Absurd claim.

>How
>        else fo you securely workout who you are supposed to be
>        communicating with.

Um.. maybe with SSL?   Check the offered certificate matches some criteria to relate it to the name and that it chains back to someplace you trust.

I'm sure there are all sorts of arguments you could make on how this isn't sufficient - but DNSSEC only at MOST gives me a validatable mapping between a domain name and the ultimate IP address - it doesn't protect against post-resolution attacks of various flavors, so I could argue DNSSEC isn't sufficient.

SSL/TLS has the nice properties that I can deploy it per server (e.g. I can get incremental benefit), that I can do off-tree validations, and that a hell of a lot of servers already implement it.  DNSSEC can't be deployed per server (requires the zone to be signed even if mostly opted out), can't do off-tree validations (DLV is a hack - I might split a hair and call it off-tree, but it really is more of a trust anchor registry than anything else), and few SMTP servers (any?) implement DNSSEC resolution/validation.




>        Mark
>-- 
>Mark Andrews, ISC
>1 Seymour St., Dundas Valley, NSW 2117, Australia
>PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org
>
>--
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From owner-namedroppers@ops.ietf.org  Mon Aug 11 13:14:30 2008
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Date: Mon, 11 Aug 2008 22:09:50 +0200
From: bert hubert <bert.hubert@netherlabs.nl>
To: "Jay R. Ashworth" <jra@baylink.com>
Cc: namedroppers@psg.com
Subject: Re: Why *can* cached DNS replies be overwritten?
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On Mon, Aug 11, 2008 at 03:04:27PM -0400, Jay R. Ashworth wrote:
> Correct me if I'm wrong, Leo, but your assertion turns on the fact that
> the server will accept an overwriting cache entry for something it
> already has cacheed, does it not?
> 
> Do djb and Power in fact do that?

Yes - PowerDNS does that because of reasons which used to be persuasive. It
is in fact probably possible to ignore such updates.

Costs are that (nameserver) changes get picked up later. 

I'll try this in PowerDNS on the several billion test queries and answers we
have to see if this breaks things.

> Everyone seems to continue asking "why can poisoning overwrite already
> cached answer" and no one seems to be answering, and, unless I'm a
> moron (which is not impossible), that's the crux of this issue.

It feels odd to deviate from 25 years of DNS practice. This may be one
reason why people find it hard to try such things.

Thanks for persistenly asking about this.

It may be something that is not theoretically allowed, but that practically
helps us out of the woods.

Will report results of the tests here.

	Bert

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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From owner-namedroppers@ops.ietf.org  Mon Aug 11 14:54:31 2008
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From: =?iso-8859-1?Q?Jesper_G._H=F8y?= <jesper@jhsoft.com>
To: "'David Conrad'" <drc@virtualized.org>
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References: <48875934.8080101@links.org> <F113C53F-D189-45A0-8DC3-14725395D1BD@virtualized.org> <20080723183227.GA11957@outpost.ds9a.nl> <028601c8f185$eeb51b90$cc1f52b0$@com> <F64EF155F05968A001280C7B@Ximines.local> <028a01c8f18c$7f6bb620$7e432260$@com> <572015C3F44995F54736D38B@Ximines.local> <029401c8f196$c5822bd0$50868370$@com> <489F0F8E.6020607@gis.net> <021101c8fb13$34634310$9d29c930$@com> <B5457C05-D2EA-4A31-94AB-84807AC62843@virtualized.org>
In-Reply-To: <B5457C05-D2EA-4A31-94AB-84807AC62843@virtualized.org>
Subject: RE: How do we get the whole world to upgrade to DNSSEC capable resolvers?
Date: Mon, 11 Aug 2008 23:47:44 +0200
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David Conrad write:
> Ignoring for the moment the fact that 134 million (or even 4 billion)
> packets isn't that much anymore (and will be less and less over time),
> the DNS lookup 'wire' is logically distinct from the content 'wire'.
> The ability to "intercept spoof" a DNS response can occur anywhere on
> the DNS lookup 'wire', not only on the content producer/consumer's
> local LAN.  By not protecting the packet content, you open yourself up
> to a distinct set of attackers beyond the local wire.

Thank you - my point exactly!
4 billion packets may not be enough - we need a longer transaction ID.
We have now come full circle to my initial post which was:

<quote>
The core problem with the Kaminsky bug, and other cache poisoning =
scenarios,
is the short 16 bit transaction ID.
So why not simply expand this ID to a secure length?
And not just ~16 bits (random ports) or 2+ bits (x020) - but really =
secure
length like 128 bits.

This seems a lot easier than getting DNSSEC in place, signing the root,
getting EVERYBODY to sign their zones, repeat for rollover, etc., etc.

Some will probably argue that this doesn't help against =
on-the-wire-attacks.
But if the bad buy is one-the-wire, then he can replace any data at will
anyway. DNSSEC is no help here.
Of course we already have SSL to solve that problem.

So why not keep DNS simple?

Am I oversimplifying matters?
</quote>


> Indeed.  DNSSEC may not be the 'only true solution' and there may be
> other solutions.  The vast majority of folks who have burned brain
> cells and stomach lining on DNSSEC could be complete idiots and an
> obvious, complete, lightweight, and architecturally clean solution
> could be staring all of us in the face.

That=92s not fair!
I most certainly never suggested anything like that.=20
I have the deepest respect for the people behind DNSSEC and all the work
that has gone into this.

But DNSSEC was not invented to fix the Kaminsky bug (the topic of this
thread).
In fact DNSSEC was invented more than 10 years earlier.

I do think it is fair to ask that other possibilities at least be =
considered
before applying something as complex as DNSSEC to this fairly simple =
problem
(short transaction ID).


Sincerely,
Jesper





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From owner-namedroppers@ops.ietf.org  Mon Aug 11 15:53:22 2008
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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers?
Date: Mon, 11 Aug 2008 15:48:34 -0700
References: <48875934.8080101@links.org> <F113C53F-D189-45A0-8DC3-14725395D1BD@virtualized.org> <20080723183227.GA11957@outpost.ds9a.nl> <028601c8f185$eeb51b90$cc1f52b0$@com> <F64EF155F05968A001280C7B@Ximines.local> <028a01c8f18c$7f6bb620$7e432260$@com> <572015C3F44995F54736D38B@Ximines.local> <029401c8f196$c5822bd0$50868370$@com> <489F0F8E.6020607@gis.net> <021101c8fb13$34634310$9d29c930$@com> <B5457C05-D2EA-4A31-94AB-84807AC62843@virtualized.org> <028c01c8fbfb$e44131a0$acc394e0$@com>
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Jesper,

On Aug 11, 2008, at 2:47 PM, Jesper G. H=F8y wrote:
> 4 billion packets may not be enough - we need a longer transaction ID.

Or, we could remove the vulnerability by protecting the data, not the =20=

transport.

> <quote>
> The core problem with the Kaminsky bug, and other cache poisoning =20
> scenarios,
> is the short 16 bit transaction ID.

No.  The core problem with the Kaminsky bug is the fact that DNS data =20=

is unprotected during transport.  Making the transaction ID bigger =20
reduces the chance of an blind insertion spoof attack, but does =20
nothing for an interception spoof attack where the attacker is in the =20=

DNS data path.  Your XTID proposal is one of a class that treats the =20
symptoms, not the underlying disease.  DNSSEC is one of a class that =20
treats the disease.  In a DNSSEC-enabled world, it wouldn't matter =20
where you got the response from or what zombie-laden networks the =20
response traversed, you would be able to validate the response hadn't =20=

been tampered with.

That isn't to say that I don't think XTID et al shouldn't be =20
considered and even implemented if they improve the status quo, but it =20=

solves a subset of the problems DNSSEC solves and as such, one has to =20=

consider whether it is superfluous, particularly as XTID (appears to) =20=

require a redeployment of both authoritative and caching servers, just =20=

like DNSSEC (and if you're going to redeploy, you're probably going to =20=

be redeploying something that is DNSSEC-capable).

> But DNSSEC was not invented to fix the Kaminsky bug (the topic of this
> thread).

Actually, it was.  Not the Kaminsky bug specifically of course, but =20
the entire class of bugs that revolve around modifying DNS data in =20
transit.

> I do think it is fair to ask that other possibilities at least be =20
> considered
> before applying something as complex as DNSSEC to this fairly simple =20=

> problem
> (short transaction ID).

First, I am unaware of anyone even suggesting that other possibilities =20=

not be considered.  On the contrary, I seem to recall pretty much =20
everyone clamoring for an alternative that provides the same level of =20=

protection as DNSSEC albeit with less =20
{development,operational,infrastructure} cost.

Second, the problem isn't that the transaction ID is too short.  The =20
short transaction ID exacerbates the problem by allowing remote =20
insertion spoofing particularly when additional section processing =20
comes into play.  The real problem is that the DNS protocol was =20
developed during a time when "be liberal in what you accept" was a =20
good idea and when nobody would intentionally muck up network data for =20=

illicit gain.  Times have changed.

Regards,
-drc


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From owner-namedroppers@ops.ietf.org  Mon Aug 11 16:51:42 2008
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers? 
In-reply-to: Your message of "Mon, 11 Aug 2008 16:03:27 -0400."
             <20080811200329.9A7A4114027@mx.isc.org> 
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> At 09:18 PM 8/10/2008, Mark Andrews wrote:
> 
> >> OK - but MX-records point to host names which point to A/AAAA records whic
> h
> >> point to IP addresses...
> >> If the bad guy is on the wire, he can intercept and replace your SMTP
> >> traffic anyway. 
> >> DNSSEC or not.
> >> 
> >> SRV-records also point to host names which...
> >
> >        DNS security is required for SMTP security to work. 
> 
> Absurd claim.

	Not really.  SMTP is not HTTPS where you know apriori which
	certificate to check for.  For SMTP you need to check the
	certificate of the mail exchanger and to find that securely
	you need DNSSEC to verify the MX record or its absence so
	you know when to use the implict MX record.

	Mark
 
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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Subject: Re: Why *can* cached DNS replies be overwritten?
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At 15:04 11/08/2008, Jay R. Ashworth wrote:
>[ cross-posted from NANOG, cause vix told me to :-)
>
>On Mon, Aug 11, 2008 at 11:20:07AM -0400, Leo Bicknell wrote:
> > If your vendor told you that you are not at risk they are wrong,
> > and need to go re-read the Kaminski paper.  EVERYONE is vunerable,
> > the only question is if the attack takes 1 second, 1 minute, 1 hour
> > or 1 day.  While possibly interesting for short term problem
> > management none of those are long term fixes.  I'm not sure your
> > customers care when .COM is poisoned if it took the attacker 1
> > second or 1 day.
>
>Correct me if I'm wrong, Leo, but your assertion turns on the fact that
>the server will accept an overwriting cache entry for something it
>already has cacheed, does it not?
>
>Do djb and Power in fact do that?
>
>If they don't, the window of opportunity to poison something like .com
>is limited to the period between when that entry expires from the local
>server's cache and the next time it hears a reply -- which will be the
>time after that expiry when someone next requests a .com name; IE
>almost immediately, no?
>
>Everyone seems to continue asking "why can poisoning overwrite already
>cached answer" and no one seems to be answering, and, unless I'm a
>moron (which is not impossible), that's the crux of this issue.
>
>Cheers,
>-- jra
>--

<no-hat>
The cynical answer is "optimization" the real answer is
"trying to be helpful".

What most/all implementations are doing is assuming that "newer" data
is better if it has the same criticality [RFC2181], this takes two forms:
if the data is identical to the existing one, the TTL on the set is extended.
If the data is different the old data is replaced.

Personally I think we need to sit down and analyze this carefully if
we are better of by outlawing/discouraging this behavior and have all
RRsets expire after the original TTL expires or do something else.

One proposal is to use the "Authority Section data for the question 
being asked" and then ask a direct query to fetch the data inserted into the
Authority section data and overwrite that with the data from Answer
section which should have higher criticality than the stuff from Authority
Section and this should prevent overwrites. (This is strictly/almost
a protocol change)

The effect of not overwriting/stretching TTL on RRsets is that
an  attacker can only poison the set of their choice once in a
while (depends on the RRset TTL and the cache's memory constraints).

<char-hat=on>
What the overall effect is going to be if caches changed this
behavior is debatable but conducting few experiments would be real
useful. Both in seeing if anything in resolution break as well as
see if this helps prevent acceptance of forgeries.

At the same time the WG should look into other approaches in this and
related spaces.

         Comments
         Olafur

   


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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers? 
In-reply-to: Your message of "Mon, 11 Aug 2008 23:47:44 +0200."
             <028c01c8fbfb$e44131a0$acc394e0$@com> 
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> But DNSSEC was not invented to fix the Kaminsky bug (the topic of this
> thread).
> In fact DNSSEC was invented more than 10 years earlier.

	Incorrect.  It was invented to protect against several
	classes of attack of which Kaminsky is just one example.

	It was assumed back when DNSSEC was originally being developed
	that someone would work out a good method for injecting
	spoofed responses.  DNSSEC was designed to deal with that
	threat.  We just hoped we would have more deployment before
	the threat became a reality.

	Mark

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PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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Subject: RE: Why *can* cached DNS replies be overwritten?
Date: Tue, 12 Aug 2008 10:31:21 +0200
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From: "Antoin Verschuren" <Antoin.Verschuren@sidn.nl>
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> -----Original Message-----
> From: owner-namedroppers@ops.ietf.org [mailto:owner-
> Subject: Why *can* cached DNS replies be overwritten?
>=20
> Do djb and Power in fact do that?

I did some investigation after my post of =
http://lists.oarci.net/pipermail/dns-operations/2008-February/002526.html=

I did not test this myself, but what people have told me is:

Dnscache, powerdns: Updates the cache by resetting the TTL if a new =
authoritative answer for the same entry is received.

Bind: Updates the cache, but only replaces the TTL with the min value

Unbound: Never updates, always waits for an entry to expire before =
accepting a new entry

> Everyone seems to continue asking "why can poisoning overwrite already
> cached answer" and no one seems to be answering, and, unless I'm a
> moron (which is not impossible), that's the crux of this issue.

I actually like the simple behavior that an authoritative answer can =
override an already cached answer.
It's efficient, and follows the simple rule that an authorative answer =
can be cached.
It only goes wrong if people don't maintain their DNS entries =
operationally, and forget to delete entries they are no longer =
authoritative for.
So the bad guys get hit.
The benefit for the good guys is that less lookups are needed, and more =
importantly, parents are hit less.
In the DNS hierarchy, you don't want every query to hit the root.
My concern is that if records always expire, like Unbound does, parent =
nameservers are hit more.

Now we can start an argument on the fact that traffic has become =
inexpensive, and root and TLD nameservers should be able to cope with =
this minimal increase in queries, but I think we should define a =
protocol to be as efficient as it can be.
I actually don't know how parent traffic will be affected, I'm =
interested to see measurements on that.
But I stay with the thought that even though we only win some bits in =
traffic, we should always aim to design a protocol to do so.

I also think we must not create protocol complexity to protect ignorant =
users from making mistakes when that does not benefit educated users.

And then there's the argument that when cached entries cannot be =
replaced, an attacker can make use of that.
"fixing" a bad cache entry remotely by sending the correct authoritative =
answer might reduce the time window a poisoned cache is operational.


Antoin Verschuren

Technical Policy Advisor
SIDN
Utrechtseweg 310
PO Box 5022
6802 EA Arnhem
The Netherlands

T +31 26 3525500
F +31 26 3525505
M +31 6 23368970
E antoin.verschuren@sidn.nl
W http://www.sidn.nl/

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From owner-namedroppers@ops.ietf.org  Tue Aug 12 05:19:05 2008
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To: Antoin Verschuren <Antoin.Verschuren@sidn.nl>
Cc: IETF DNSEXT WG <namedroppers@ops.ietf.org>
Subject: Dealing with the NS RRSet [Re: Why *can* cached DNS replies be overwritten?]
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On Tue, Aug 12, 2008 at 10:31:21AM +0200, Antoin Verschuren wrote:

> I actually like the simple behavior that an authoritative answer can override an already cached answer.
> It's efficient, and follows the simple rule that an authorative answer can be cached.

well, I had read your earlier comments slightly differently, especially
w.r.t. the "name server lock-in" problem.

> It only goes wrong if people don't maintain their DNS entries operationally, and forget to delete entries they are no longer authoritative for.

... or aren't informed or don't cooperate for other reasons. We know how to
gracefully migrate from one NS RRSet do another, even disjoint, one,
but we also know that this migration doesn't really happen that often
in today's mass hosting environments.  But can catch two birds with one
stone here, I believe:

Let's see what different flavors the forged responses can have:

-----------------------------------------------------------------------------
;; QUESTION SECTION:
;345678.example.org.		IN	A

;; ANSWER SECTION:
345678.example.org.        3600	IN	A	192.0.2.1

;; AUTHORITY SECTION:
example.org.               3600	IN	NS      ns1.example.org.
example.org.               3600	IN	NS	ns2.example.net.

;; ADDITIONAL SECTION:
ns1.example.org.           3600	IN	A	10.0.0.42
www.example.org.           3600	IN	A	192.0.2.80
-----------------------------------------------------------------------------

Unsolicited additional information should already be ignored and data
from the additional section shouldn't overwrite a (previous) authoritative
answer as per RFC 2181. 0 points.

-----------------------------------------------------------------------------
;; QUESTION SECTION:
;345678.example.org.		IN	A

;; ANSWER SECTION:
345678.example.org.        3600	IN	A	192.0.2.1

;; AUTHORITY SECTION:
example.org.               3600	IN	NS      www.example.org.
example.org.               3600	IN	NS	ns2.example.net.

;; ADDITIONAL SECTION:
www.example.org.           3600	IN	A	192.0.2.80
-----------------------------------------------------------------------------

The additional section data is logically justified, but RFC 2181 helps.
0 points.

-----------------------------------------------------------------------------
;; QUESTION SECTION:
;345678.example.org.		IN	A

;; ANSWER SECTION:
345678.example.org.        3600	IN	A	192.0.2.1

;; AUTHORITY SECTION:
example.org.               3600	IN	NS      evil1.example.net.
example.org.               3600	IN	NS      evil2.example.net.
-----------------------------------------------------------------------------

Now, to have gotten here, the resolver has already followed a referral.
In theory, the referral and the authoritative data are always in sync,
so there's no need to replace one with the other. In practice, though,
the authoritative NS RRSet is the more credible one.
Distinguish between a referral NS RRSet and an "authoritative" NS RRSet
(quotes because it stems from the authoritative source, but isn't
formally covered by the AA bit):  let the latter _only_ overwrite the
former.  This brings back the window of opportunity whose size is
determined by the TTL of the "authoritative" NS RRSet.

However, there's a remaining risk here at those levels where a positive
authoritative response does not normally occur under normal operations,
most prominently most of the TLDs.

-----------------------------------------------------------------------------
;; QUESTION SECTION:
;345678.example.org.		IN	A

;; ANSWER SECTION:
345678.example.org.        3600	IN	A	192.0.2.1

;; AUTHORITY SECTION:
example.org.               3600	IN	NS      345678.example.org.
-----------------------------------------------------------------------------

Same as above. It's the NS RRSet, not the address data.

> In the DNS hierarchy, you don't want every query to hit the root.
> My concern is that if records always expire, like Unbound does, parent nameservers are hit more.

Sure, but this is hard to predict. It depends on the relation of TTLs
between both NS RRSets as well as the TTLs of the authoritative NS RRSet
and the TTL of the data you're actually interested in.

But, isn't the phantom referral the really hard one:
-----------------------------------------------------------------------------
;; QUESTION SECTION:
;345678.www.example.org.		IN	A

;; AUTHORITY SECTION:
www.example.org.           3600	IN	NS      evil1.example.net.
www.example.org.           3600	IN	NS      evil2.example.net.
-----------------------------------------------------------------------------

What are mitigation techniques here?

o let the resolver remember the (potentially invisible) zone cut
o expire all RRSets atthe same owner at once (bad effect on the parent)
o really delegate at every level (have fun with IP6.ARPA and ENUM)
o ...

-Peter

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 overwritten?]
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On Tue, 12 Aug 2008, Peter Koch wrote:
>
> Let's see what different flavors the forged responses can have:

Now about

;; QUESTION SECTION:
;345678.example.org.		IN	A

;; ANSWER SECTION:
345678.example.org.	3600	IN	CNAME	www.example.org.
www.example.org.	3600	IN	A	192.0.2.80	; evil

Tony.
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As mentioned during the WG meeting in Dublin, we would like draft 
"Signaling Cryptographic Algorithm Understanding in DNSSEC" to become a 
working group document.

the latest version is in the ID database:
https://datatracker.ietf.org/drafts/draft-crocker-dnssec-algo-signal/


Comments welcome (as always).  Please send nits/edits/typos directly to 
the authors (Steve Crocker and me).

Thanks,
Scott

-- 
----------------------------------------
Scott Rose            Computer Scientist
NIST
ph: +1 301-975-8439
scott.rose@nist.gov

http://www-x.antd.nist.gov/dnssec
http://www.dnsops.gov/
-----------------------------------------

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From owner-namedroppers@ops.ietf.org  Tue Aug 12 07:06:20 2008
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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable 
 resolvers? 
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On Mon, 11 Aug 2008, Michael StJohns wrote:
>
> SSL/TLS has the nice properties that I can deploy it per server (e.g. I
> can get incremental benefit), that I can do off-tree validations, and
> that a hell of a lot of servers already implement it.

It has the problem that a large proportion of MXs that offer TLS have the
wrong certificate, so you can't easily turn on certificate verification
for your outgoing email. There's essentially no requirement for
certificate verification in the specification, nor is it clear exactly
which domain you are supposed to compare against any certificate.

Tony.
-- 
f.anthony.n.finch  <dot@dotat.at>  http://dotat.at/
NORTH UTSIRE SOUTH UTSIRE: SOUTHEASTERLY 4, BACKING NORTHEASTERLY 5 TO 7 FOR A
TIME. MODERATE OR ROUGH. RAIN OR SHOWERS. MODERATE OR GOOD, OCCASIONALLY POOR.

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From owner-namedroppers@ops.ietf.org  Tue Aug 12 07:47:59 2008
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To: lendl@nic.at
Cc: namedroppers@ops.ietf.org
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS
From: Havard Eidnes <he@uninett.no>
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>   * Are there any open protocol issues which make such a
>     "single checkbox" deployment of DNSSEC impossible?

The need to communicate off-line or at least out-of-protocol with
the parent zone administrator when you need to change/roll-over your
KSKs -- this is probably what you meant by "automatic DS generation
in the parent" in your next item.  Although this might be seen as
similar to making changes to the NS RRset, the initiative is
triggered by a timer and not by administrator action, which is a
considerable change from previous operational practice.

There's also the issue of trust anchor maintenance, but that's being
worked on, as I understand it.

When reading some of the DNSSEC RFCs, I've sometimes come away with the=

understanding that the authors think that "zone administrators needs to=

sign the zone on an off-line machine to maintain a sufficiently high
level of security".  If I've understood correctly, that's completely at=

odds with the goal of having a fully automated feature with a checkbox
for "maintain (generate and periodically roll) ZSKs and KSKs and sign
and re-sign all my zones automatically".  My guess is that only TLD and=

root zone maintainers would care enough about their zones and keys to
bear the level of pain involved in implementing complete off-line
signing ("zone transfer via sneakernet").  For a simple leaf zone maste=
r
name server administrator, is there a good reason he needs to care more=

about his DNS private keys than about the protection and host security
on the master name server (which might be "hidden", i.e. not in the NS
set)?  (OK, that probably wasn't a protocol issue...)

Then there's the aspect of having the root signed, which is really
needed in order to alleviate the pain of maintaining the trust
anchors, a pain which is to be felt on all the recursive name servers
who want to get the benefits of DNSSEC.  Even if it appears to be a
non-protocol issue does not make it any less important in the view of
deployment.

Best regards,

- H=E5vard

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From owner-namedroppers@ops.ietf.org  Tue Aug 12 08:11:17 2008
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers? 
In-reply-to: Your message of "Tue, 12 Aug 2008 14:59:53 +0100."
             <alpine.LSU.1.10.0808121452401.19189@hermes-1.csi.cam.ac.uk> 
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> On Mon, 11 Aug 2008, Michael StJohns wrote:
> >
> > SSL/TLS has the nice properties that I can deploy it per server (e.g. I
> > can get incremental benefit), that I can do off-tree validations, and
> > that a hell of a lot of servers already implement it.
> 
> It has the problem that a large proportion of MXs that offer TLS have the
> wrong certificate, so you can't easily turn on certificate verification
> for your outgoing email.  There's essentially no requirement for
> certificate verification in the specification, nor is it clear exactly
> which domain you are supposed to compare against any certificate.

	The certificate should match the host name in the reply to
	the HELO message which should in turn also match EXCHANGE
	in the MX record in the general case.

	Checking the later part was specified in RFC 821 Section
	3.5. OPENING AND CLOSING.

      "At the time the transmission channel is opened there is an
      exchange to ensure that the hosts are communicating with the
      hosts they think they are."

	The former is a logical extension.

	Mark

> Tony.
> -- 
> f.anthony.n.finch  <dot@dotat.at>  http://dotat.at/
> NORTH UTSIRE SOUTH UTSIRE: SOUTHEASTERLY 4, BACKING NORTHEASTERLY 5 TO 7 FOR 
> A
> TIME. MODERATE OR ROUGH. RAIN OR SHOWERS. MODERATE OR GOOD, OCCASIONALLY POOR
> .
> 
> --
> to unsubscribe send a message to namedroppers-request@ops.ietf.org with
> the word 'unsubscribe' in a single line as the message text body.
> archive: <http://ops.ietf.org/lists/namedroppers/>
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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To: Havard Eidnes <he@uninett.no>
Cc: lendl@nic.at, namedroppers@ops.ietf.org
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: OFFTOPIC: DNSSEC groupthink versus improving DNS 
In-reply-to: Your message of "Tue, 12 Aug 2008 16:40:48 +0200."
             <20080812.164048.246546894.he@uninett.no> 
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> >   * Are there any open protocol issues which make such a
> >     "single checkbox" deployment of DNSSEC impossible?
> 
> The need to communicate off-line or at least out-of-protocol with
> the parent zone administrator when you need to change/roll-over your
> KSKs -- this is probably what you meant by "automatic DS generation
> in the parent" in your next item.  Although this might be seen as
> similar to making changes to the NS RRset, the initiative is
> triggered by a timer and not by administrator action, which is a
> considerable change from previous operational practice.

Which, in practice, may not be necessary though I would expect that
TLD's will continue to rollover keys

For end user zones the only key roll overs may be emergency key
rollovers.
 
> There's also the issue of trust anchor maintenance, but that's being
> worked on, as I understand it.
> 
> When reading some of the DNSSEC RFCs, I've sometimes come away with the=
> 
> understanding that the authors think that "zone administrators needs to=
> 
> sign the zone on an off-line machine to maintain a sufficiently high
> level of security".  If I've understood correctly, that's completely at=
> 
> odds with the goal of having a fully automated feature with a checkbox
> for "maintain (generate and periodically roll) ZSKs and KSKs and sign
> and re-sign all my zones automatically".  My guess is that only TLD and=
> 
> root zone maintainers would care enough about their zones and keys to
> bear the level of pain involved in implementing complete off-line
> signing ("zone transfer via sneakernet").  For a simple leaf zone maste=
> r
> name server administrator, is there a good reason he needs to care more=
> 
> about his DNS private keys than about the protection and host security
> on the master name server (which might be "hidden", i.e. not in the NS
> set)?  (OK, that probably wasn't a protocol issue...)

The protocol had to support completely offline keys.   The actual
practice is up to the zone administrator.
 
> Then there's the aspect of having the root signed, which is really
> needed in order to alleviate the pain of maintaining the trust
> anchors, a pain which is to be felt on all the recursive name servers
> who want to get the benefits of DNSSEC.  Even if it appears to be a
> non-protocol issue does not make it any less important in the view of
> deployment.

But it's lack isn't a show stopper either.
 
> Best regards,
> 
> - H=E5vard
> 
> --
> to unsubscribe send a message to namedroppers-request@ops.ietf.org with
> the word 'unsubscribe' in a single line as the message text body.
> archive: <http://ops.ietf.org/lists/namedroppers/>
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

--
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From: Edward Lewis <Ed.Lewis@neustar.biz>
Subject: transfering vs. loading a zone
Cc: ed.lewis@neustar.biz
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During the DNSEXT meeting at IETF 72 one topic came up regarding the 
"AXFR clarify" draft.  The topic is "the difference between a zone 
transfer and zone load operation."

The issue begins with the question "what is in a zone?"  That 
question is what derailed the document a half decade ago.  The 
question is not that easy to answer.

There is a statement in the original RFCs about what is in a zone, 
and the statement is pretty clear.  However, the advent of dynamic 
update (with the ability to add a cut point) created a class of 
records now called "obscured records" and this class gained 
additional importance with the advent of DNAME.

Obscured records are not the first records which can be classified as 
"wrong" but are legitimately tied to a zone, earlier examples of this 
are "bad" glue records, i.e., glue record with different address(es) 
than the authoritative data they represent.

Complicating matters, once we recognize that bad glue and obscured 
records are legitimate parts of a zone, through the fact that the 
records were added by the administrator, what about "typos?"  Of 
course, a typo of transposing bits in a AAAA record is something the 
DNS itself won't know about, but a typo like:


     $ORIGIN example.
     @              SOA        ...
     <...>
     ns1.nic        AAAA       3ffe::1
     ns1.nic.       A          127.0.0.1

The AAAA shown is for ns1.nic.example. and the A is ns1.nic.  Is the 
address record for ns1.nic. in the zone even though this might make a 
name server refuse to load and serve the zone?

This raises the issue - what is in a zone?  I see three possible 
(extreme) answers:

1.) Exactly what the administrator places into the zone.
2.) The subset of #1 excluding typos.
3.) The best data that should be there.

If #1 is done perfectly right, then all three are the same.

Why not #3?  If the nameservers start editing the zone, 
troubleshooting becomes troublesome.  From personal experience, I 
knew of an erstwhile zone that had many, many lame delegations.  Most 
servers for the zone also served all of the children, meaning it was 
hard to capture the lame delegations.  But one server exposed the 
lame delegations and that was causing operational problems. 
Fortunately, as an operator of a slave for the zone I got a copy of 
the zone via AXFR and was able to debug and alert the admin.

It pays to let errors become exposed.  Makes debugging easier.  Of 
course, covering over bumps is good - if all the covering is done the 
same way.  In an interoperable world though, nothing is always "done 
the same way."

A comment was made at the mic in the meeting that we should think of 
a zone "for a particular serial number."  And the zone for a 
particular serial number is "set in stone" when the zone is 
successfully loaded at the master server.  Not by the administrator, 
and zones that fail to load never get to be that version.  This is 
because only after the master loads the zone will either there be 
NOTIFYs sent or the slaves will poll and see the incremented serial 
number.  If any name server, especially the master, "edits" the zone 
(that is loads a subset of what is given), the name server has taken 
an editing pen to the administrator's work.

Why not #2?  It isn't clear if typo errors are objectively defined. 
I haven't thought all the way through but my hunch is that trying to 
algorithmically decide if a mistake was made is nearly impossible.

So that leaves #1, "warts and all."  In my opinion, it's the right 
approach, but then again this is an opinion to be expressed by the 
working group.

But let's assume for now a zone is defined as #1, and press on to the 
issue of loading a zone (from an AXFR - as AXFR is the topic at hand).

If an AXFR will deliver to a name server the contents of a zone 
according to the criteria of #1 above, the name server ought to do 
some sanity checking on it.  I.e., the zone is not #3, it is not 
ready for immediate consumption.

A name server could parse the zone and decide not to serve it due to 
errors.  A name server has to recognize the "obscured" (or "occluded" 
I forget the term we want to use) records.

Here's an open question.  If a name server gets a zone via AXFR 
(presumably the name server had a reason to ask for it) and decides 
the zone is bad and returns SERVFAIL to all queries for data in the 
zone, will the name server still store the zone, send NOTIFYs and 
serve it as AXFR/IXFR?

Is it possible for a name server to hold a cache of zones that failed 
to load?  I mean, one failed load per zone configured, not a running 
history.

Is the decision to transfer a zone different from the decision to 
load and serve a zone?

This is meant to start an open discussion...so maybe this isn't all 
wrapped up, but I'm seeking comments.  Eventually this will be in a 
section about the differences between AXFR and loading.
-- 
-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-
Edward Lewis                                                +1-571-434-5468
NeuStar

Never confuse activity with progress.  Activity pays more.

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From owner-namedroppers@ops.ietf.org  Tue Aug 12 09:11:42 2008
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Date: Tue, 12 Aug 2008 18:02:35 +0200
From: Otmar Lendl <lendl@nic.at>
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Subject: DNSSEC on autopilot (was: OFFTOPIC: DNSSEC groupthink versus improving
 DNS)
References: <489B09FE.8050701@e164.org>	<49451.1218124457@nsa.vix.com>	<489C5202.4080405@nic.at> <20080812.164048.246546894.he@uninett.no>
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Havard Eidnes wrote:
>>   * Are there any open protocol issues which make such a
>>     "single checkbox" deployment of DNSSEC impossible?
> 
> The need to communicate off-line or at least out-of-protocol with
> the parent zone administrator when you need to change/roll-over your
> KSKs -- this is probably what you meant by "automatic DS generation
> in the parent" in your next item.

RFC 5011 offers a way to do key rollover without out-of-protocol 
interactions, as well as most other common trust anchor operations.

The intention of 5011 certainly wasn't "parent to child" but "island
to island" secure entry point management.

I'm in brainstorming mode, so: Why can't 5011 be used by TLDs instead of
extending the Registry/Registrar protocol? That change takes time
and puts the Registrar into the critical path for DNSSEC rollout.

Yes, this can be 100% automatic: a test-signing of a zone should not
automatically result in a signed DS in the parent, which could prove
fatal if the zone reverts to being unsigned. But couple it with an email
loop "We have detected your key, do you want us to include DS records in
the TLD zone? Please click YES or NO" to the domain owner this might
be "good enough".

> When reading some of the DNSSEC RFCs, I've sometimes come away with the
> understanding that the authors think that "zone administrators needs to
> sign the zone on an off-line machine to maintain a sufficiently high
> level of security". 

Correct, and that makes a lot of sense for TLDs and domains used for 
e-commerce.

 > If I've understood correctly, that's completely at
> odds with the goal of having a fully automated feature with a checkbox
> for "maintain (generate and periodically roll) ZSKs and KSKs and sign
> and re-sign all my zones automatically".  My guess is that only TLD and
> root zone maintainers would care enough about their zones and keys to
> bear the level of pain involved in implementing complete off-line
> signing ("zone transfer via sneakernet").  For a simple leaf zone master
> name server administrator, is there a good reason he needs to care more
> about his DNS private keys than about the protection and host security
> on the master name server (which might be "hidden", i.e. not in the NS
> set)?  (OK, that probably wasn't a protocol issue...)

Just look at how people deal with SSL and ssh server keys. I guess less 
than 5% of the https: sites don't have the key (+passphrase, if any) on the 
webserver. (Back in my old job, when SSL was new, we had to enter the 
passphrase on server reboots/restarts. What a hassle. I strongly doubt this
is still done in most installations.)

ssh server keys? I have yet to see a server that doesn't store them on 
disk. (IIRC, the sshd server even regenerates temporary server keys every
few hours. This completely transparent to the admin and user.)

So no, I don't think that your average name server admin will care more
about his dnssec keys than the overall security of this servers.

For ssh, the "ask on first contact, store and YELL if it changes"-security 
model seems to be really popular. Phil Zimmerman's zPhone uses the same idea.

Can't the same principle work for DNSSEC child->parent provisioning?

> Then there's the aspect of having the root signed, which is really
> needed in order to alleviate the pain of maintaining the trust
> anchors, a pain which is to be felt on all the recursive name servers
> who want to get the benefits of DNSSEC.  Even if it appears to be a
> non-protocol issue does not make it any less important in the view of
> deployment.

Getting the root signed is, of course, the jackpot.

If we can get the registry/registrar interface and the registrar/customer 
interface out of the critical path, that might make getting TLDs 
DNSSEC-enabled a lot easier and thus faster. If TLDs get serious with 
DNSSEC, then the task of secure entry point management for resolvers 
becomes a *lot* easier.

Once again, from a pure protocol point of view, is 5011 enough to cut
out the registrar from the DNSSEC provisioning loop?

I'm sure there are pitfalls (e.g. how to handle emergency key rollovers).

/ol
-- 
// Otmar Lendl <lendl@nic.at>, T: +43 1 5056416 - 33, F: - 933 //

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From owner-namedroppers@ops.ietf.org  Tue Aug 12 09:46:20 2008
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Date: Tue, 12 Aug 2008 09:40:07 -0700
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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable
 resolvers?
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At 11:18 +1000 8/11/08, Mark Andrews wrote:

>	DNS security is required for SMTP security to work.

That is why the SIKED (Secure Internet KEy Distribution) BoF failed, 53rd IETF.

If SMTP security works because DNS security works, then a DNS 
security failure means SMTP security fails too.  A house of cards. 
This is what is feared.

(see also http://www.potaroo.net/ietf/idref/draft-lewis-siked-dnsargs/)

Thanks to Geoff Huston for maintaining that repository.  Although I'd 
call it "Pandora's Box" because of all of the bad ideas documented in 
there that never mad it to RFC. ;)
-- 
-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-
Edward Lewis                                                +1-571-434-5468
NeuStar

Never confuse activity with progress.  Activity pays more.

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Subject: Re: DNSSEC on autopilot (was: OFFTOPIC: DNSSEC groupthink versus
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[no hat]

On Tue, Aug 12, 2008 at 06:02:35PM +0200, Otmar Lendl wrote:

> I'm in brainstorming mode, so: Why can't 5011 be used by TLDs instead of
> extending the Registry/Registrar protocol? That change takes time
> and puts the Registrar into the critical path for DNSSEC rollout.

In at least some cases, two reasons:

1.  The EPP extension for DS management has been ready for ages.  So
there's very little work to do there anyway.  It's in RFC 4310.  (Of
course, some registries aren't using EPP, so it's not relevant to them.)

2.  Many TLDs aren't actually allowed to talk to the party that has
administrative control of the domain.  In the ICANN world, for
instance, registries may only speak to the registrar, and not the
registrant.  This is admittedly a policy and not a technical reason,
but it's a reason anyway.

A

-- 
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From: Florian Weimer <fweimer@bfk.de>
Date: Tue, 12 Aug 2008 18:55:02 +0200
In-Reply-To: <alpine.LSU.1.10.0808121435400.19189@hermes-1.csi.cam.ac.uk> (Tony Finch's message of "Tue, 12 Aug 2008 14:38:22 +0100")
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* Tony Finch:

> On Tue, 12 Aug 2008, Peter Koch wrote:
>>
>> Let's see what different flavors the forged responses can have:

Thanks for posting this summary.

> Now about
>
> ;; QUESTION SECTION:
> ;345678.example.org.		IN	A
>
> ;; ANSWER SECTION:
> 345678.example.org.	3600	IN	CNAME	www.example.org.
> www.example.org.	3600	IN	A	192.0.2.80	; evil

IIRC, it has been argued that the AA bit only applies to the top-most
CNAME (or the record whose name matches the QNAME, forgot whih).
Based on that, RFC 2181 rules would prevent a cache override.

There are a few more things.  First, using RCODE=3D3 to clear the cache:

| ;; ->>HEADER<<- opcode: QUERY, status: NXDOMAIN, id: 39020
|=20
| ;; QUESTION SECTION:
| ;www.example.org.		IN	TYPE1337 ; varies
=20
followed by:
=20
| ;; QUESTION SECTION:
| ;www.example.org.               IN      A
|=20
| ;; ANSWER SECTION:
| www.example.org.      3600    IN      A       192.0.2.80      ; evil

>From a statistical point of view, this is less interesting because it
requires spoofing in quick succession.  It doesn't work against all
implementations, either.  I don't think it's covered by RFC 2181.

The other approach is:

| ;; QUESTION SECTION:
| ;www.example.org.               IN      TYPE1337 ; varies
|=20
| ;; ANSWER SECTION:
| www.example.org.      3600    IN      CNAME evil.example.net.

Again, the effectiveness of this trick depends heavily on the cache
implementation.  Some might have a RTYPE-specific CNAME cache, some
might throw away the existing A record once they encounter the CNAME,
some may prefer the existing record, until it expires from the cache,
when they start using the CNAME.  (The wording I suggested for the
DNAME draft assumes that the CNAME caching rules are updated to
address this.)

I think the following has already been mentioned?

| ;; QUESTION SECTION:
| ;235223.example.org.               IN      MX
|=20
| ;; ANSWER SECTION:
| 235223.example.org.      3600    IN      MX 10   www.example.org.
|
| ;; ADDITIONAL SECTION:
| www.example.org.         3600    IN      A  192.0.2.80 ; evil

Again, RFC 2181 should cover this.  Anything else with additional
section processing is affected in a similar way (and should be treated
similarly).

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=DFe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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To: Olafur Gudmundsson <ogud@ogud.com>
cc: "Jay R. Ashworth" <jra@baylink.com>, namedroppers@psg.com
In-Reply-To: Your message of "Mon, 11 Aug 2008 20:32:48 -0400."
             <200808120032.m7C0WqNc078602@stora.ogud.com> 
References: <20080811190427.GD9082@cgi.jachomes.com>  <200808120032.m7C0WqNc078602@stora.ogud.com> 
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nonreplacement of rrsets is not a general fix.  there are plenty of kaminsky
message patterns that rely only on insertion of new data.  so while i'm having
great fun with just reducing the TTL when a replacement is attempted, 
especially with NS RRsets, it doesn't make me safe.

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Date: Tue, 12 Aug 2008 19:10:24 +0200
From: Peter Koch <pk@DENIC.DE>
To: IETF DNSEXT WG <namedroppers@ops.ietf.org>
Subject: Re: Dealing with the NS RRSet [Re: Why *can* cached DNS replies be overwritten?]
Message-ID: <20080812171024.GH39395@unknown.office.denic.de>
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On Tue, Aug 12, 2008 at 02:38:22PM +0100, Tony Finch wrote:

> Now about

not NS RRSet based, but still ...

> ;; QUESTION SECTION:
> ;345678.example.org.		IN	A
> 
> ;; ANSWER SECTION:
> 345678.example.org.	3600	IN	CNAME	www.example.org.
> www.example.org.	3600	IN	A	192.0.2.80	; evil

Can be mitigated two ways:

1) do not believe anything after the (first) CNAME RR (DNAME with CNAME
   synthesis needs special consideration)

2) again, do not overwrite anything in the cache, unless the new
   response is _more_ credible (as opposed to "greater or equal")

-Peter

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From owner-namedroppers@ops.ietf.org  Tue Aug 12 11:26:49 2008
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Date: Tue, 12 Aug 2008 20:15:39 +0200
From: Peter Koch <pk@DENIC.DE>
To: IETF DNSEXT WG <namedroppers@ops.ietf.org>
Subject: Re: WGLC summary for draft-ietf-dnsext-forgery-resilience
Message-ID: <20080812181539.GJ39395@unknown.office.denic.de>
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On Wed, Jul 30, 2008 at 09:29:07PM +0200, bert hubert wrote:

> I've updated chapter 9 as outlined in the posting by Andrew, plus addressed
> all nits Peter Koch had open.

I've read -06 and the diffs and thank Bert for patiently addressing all these
editorial issues. New nit in new section 9.2.1: "DNS ID" isn't consistently
used throughout the document; that can be fixed through RFC Editor work,
or might not even be ambiguous.

> Jinmei. Additionally, Peter Koch told me he sent me an example which would
> fit well in the draft, but I can't find it, but I did promise I'd include
> it.

The example appears as a comment to section 6 in
<http://www.ops.ietf.org/lists/namedroppers/namedroppers.2008/msg00695.html>.

However, in the light of recent events and also since section 6 addresses
a different threat than the rest of teh recommendation, I'm no longer
sure it is helpful (although examples in general are ;-)

-Peter

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From owner-namedroppers@ops.ietf.org  Tue Aug 12 14:16:10 2008
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Date: Tue, 12 Aug 2008 23:03:39 +0200
From: Otmar Lendl <lendl@nic.at>
To: Andrew Sullivan <ajs@commandprompt.com>
Cc: namedroppers@ops.ietf.org
Subject: Re: DNSSEC on autopilot (was: OFFTOPIC: DNSSEC groupthink versus improving DNS)
Message-ID: <20080812210339.GA23393@nic.at>
References: <489B09FE.8050701@e164.org> <49451.1218124457@nsa.vix.com> <489C5202.4080405@nic.at> <20080812.164048.246546894.he@uninett.no> <48A1B41B.1060707@nic.at> <20080812164603.GA27562@commandprompt.com>
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On 2008/08/12 18:08, Andrew Sullivan <ajs@commandprompt.com> wrote:
> On Tue, Aug 12, 2008 at 06:02:35PM +0200, Otmar Lendl wrote:
> 
> > I'm in brainstorming mode, so: Why can't 5011 be used by TLDs instead of
> > extending the Registry/Registrar protocol? That change takes time
> > and puts the Registrar into the critical path for DNSSEC rollout.
> 
> In at least some cases, two reasons:
> 
> 1.  The EPP extension for DS management has been ready for ages.  So
> there's very little work to do there anyway.  It's in RFC 4310.  (Of
> course, some registries aren't using EPP, so it's not relevant to them.)

It's not the protocol extension specification, which is the problem.
It's getting the registrars to actually implement it and support it in
their customer-facing interfaces. Bringing the registrar into the loop
also might means legal work: T&Cs, liability questions, ...

> 2.  Many TLDs aren't actually allowed to talk to the party that has
> administrative control of the domain.  In the ICANN world, for
> instance, registries may only speak to the registrar, and not the
> registrant.  This is admittedly a policy and not a technical reason,
> but it's a reason anyway.

Acknowledged, but luckily that doesn't apply to .at.

/ol
-- 
// Otmar Lendl <lendl@nic.at>, T: +43 1 5056416 - 33, F: - 933
// nic.at Internet Verwaltungs- und Betriebsgesellschaft m.b.H
// http://www.nic.at/  LG Salzburg, FN 172568b, Sitz: Salzburg

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To: Edward Lewis <Ed.Lewis@neustar.biz>
Cc: namedroppers@ops.ietf.org
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers? 
In-reply-to: Your message of "Tue, 12 Aug 2008 09:40:07 MST."
             <a06240800c4c76ac5cf38@[0.0.0.0]> 
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> At 11:18 +1000 8/11/08, Mark Andrews wrote:
> 
> >	DNS security is required for SMTP security to work.
> 
> That is why the SIKED (Secure Internet KEy Distribution) BoF failed, 53rd IET
> F.
> 
> If SMTP security works because DNS security works, then a DNS 
> security failure means SMTP security fails too.  A house of cards. 
> This is what is feared.

Lots of things really depend on DNS working as intended.  I'm just
sick and tired of all those who think that hop by hop security is
enough for the DNS.  It isn't and it never has been.

It is time to put the little bit of effort into creating DNSKEY's
and signing your zones.  It really isn't a big operational effort
that everyone keeps saying it is without actually attempting to
do it.

> (see also http://www.potaroo.net/ietf/idref/draft-lewis-siked-dnsargs/)
> 
> Thanks to Geoff Huston for maintaining that repository.  Although I'd 
> call it "Pandora's Box" because of all of the bad ideas documented in 
> there that never mad it to RFC. ;)
> -- 
> -=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-
> Edward Lewis                                                +1-571-434-5468
> NeuStar
> 
> Never confuse activity with progress.  Activity pays more.
> 
> --
> to unsubscribe send a message to namedroppers-request@ops.ietf.org with
> the word 'unsubscribe' in a single line as the message text body.
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-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Tue Aug 12 15:52:42 2008
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From: Edward Lewis <Ed.Lewis@neustar.biz>
Subject: DNSSEC and alternatives
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I've partly read the threads on the Kaminsky "bug" and how DNSSEC is 
either the savior or, possibly in alliance with the bug, devil 
incarnate.

First, to those that believe DNSSEC is an ugly pig, an ugly hack, I 
say you are wrong.  DNSSEC was carefully designed to protect the DNS 
from the threats of cache poisoning, in general, against the spoofing 
of records between an authoritative server and anything doing the 
asking.

Second to those that are skeptical of deploying DNSSEC, I say you are 
right.  Even if DNSSEC is good technology, that doesn't mean it 
should be pressed into service.

And to those of you who think you can build a "better mousetrap" I 
encourage you.  But is isn't a race against DNSSEC, it's a race 
against the vulnerabilities in DNS.  And remember - if the solution 
comes to mind easily, someone else before you probably has already 
thought it and tried it, so don't be disappointed if everyone else is 
skeptical of the new mousetrap.

The problem with DNSSEC is that it has no problems.  If it had a 
defect that prevented its adoption, then there would be something to 
engineer.  The problem with DNSSEC is not it, but that the situation 
for which it was designed doesn't need it badly enough to employ it.

                              ---------------------

Each part of the DNSSEC design was carefully considered.  There were 
many design choices made, many alternate solutions tossed aside.  The 
current definition is the third incarnation of the protocol to be 
defined in RFCs.

In about 2004 there was a push that culminated in the NSEC3 RFC.  At 
that time I posted a message going over the design decisions that 
gave us the NSEC record. (See 
http://ops.ietf.org/lists/namedroppers/namedroppers.2004/msg01406.html) 
Read that message to see the conscious design decision process.  We 
had to give something up to eliminate zone enumeration to arrive at 
what is now called NSEC3.

DNSSEC is not the problem.  It is what it is.  It is a solution to 
the problem of spoofed data.  It values completeness in security, 
compatibility with operations, at the cost of having to maintain a 
key infrastructure.  For those that get hung up on the off-line, 
air-gapped key, that is a vestige of the time the Security Area 
managed the development of the protocol (DNSSEC WG days), it really 
isn't important at all to operations.  Personally I think and have 
always thought it was overkill.

DNSSEC has taken time, a long time, to develop.  Why is this usually 
cast as a negative comment?  The time spent to generate the 
extensions is a sign of the careful consideration that went into it. 
The reason for three iterations is that we workshopped the technology 
over and over and rethought where it stunk.  At least it was never 
rushed into service.

For all the platitudes I am laying at the feet of DNSSEC, my recent 
presentations have been anti-DNSSEC.  There are presentations at 
APTLD in February and a CENTR meeting floating around which I won't 
post the URL for here.  My anti-DNSSEC sentiment is not about the 
technology, my anti-ness is about whether the problems it solves are 
important enough to solve at that cost or whether there is a cheaper 
(less op-ex) means to attain the same protection.  Or, extending the 
last, cheaper while attaining a sufficient but lesser level (sliding 
scale) of protection.

I've witnessed the DNSSEC deployment process from its beginning (with 
the publishing of RFC 2065) to now, from the first meeting at IETF 41 
where the funding for BIND 9 began to appear.  (Doing the math, IETF 
72 - IETF 41 = 31, 31/(3/year) = 10.333333333 years.  More than a 
decade now.)  I was there when the process consisted of workshops, 
tutorials, code fixes, protocol fixes, supplemental documentation, 
tools, more additions, rewrites, etc.  All of this succeeded in 
developing a workable extension to DNS, compatible with the 
underlying protocol but still a boatload of operational work.

Perhaps in order to understand DNSSEC you have to join the 
"groupthink" mind-meld.  And that would be a problem.

-- 
-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-
Edward Lewis                                                +1-571-434-5468
NeuStar

Never confuse activity with progress.  Activity pays more.

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From owner-namedroppers@ops.ietf.org  Tue Aug 12 16:12:43 2008
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To: Edward Lewis <Ed.Lewis@neustar.biz>
Cc: namedroppers@ops.ietf.org
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: transfering vs. loading a zone 
In-reply-to: Your message of "Tue, 12 Aug 2008 08:25:46 MST."
             <a06240800c4c752b74d81@[192.168.50.50]> 
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> During the DNSEXT meeting at IETF 72 one topic came up regarding the 
> "AXFR clarify" draft.  The topic is "the difference between a zone 
> transfer and zone load operation."
> 
> The issue begins with the question "what is in a zone?"  That 
> question is what derailed the document a half decade ago.  The 
> question is not that easy to answer.
> 
> There is a statement in the original RFCs about what is in a zone, 
> and the statement is pretty clear.  However, the advent of dynamic 
> update (with the ability to add a cut point) created a class of 
> records now called "obscured records" and this class gained 
> additional importance with the advent of DNAME.
> 
> Obscured records are not the first records which can be classified as 
> "wrong" but are legitimately tied to a zone, earlier examples of this 
> are "bad" glue records, i.e., glue record with different address(es) 
> than the authoritative data they represent.
> 
> Complicating matters, once we recognize that bad glue and obscured 
> records are legitimate parts of a zone, through the fact that the 
> records were added by the administrator, what about "typos?"  Of 
> course, a typo of transposing bits in a AAAA record is something the 
> DNS itself won't know about, but a typo like:
> 
> 
>      $ORIGIN example.
>      @              SOA        ...
>      <...>
>      ns1.nic        AAAA       3ffe::1
>      ns1.nic.       A          127.0.0.1
> 
> The AAAA shown is for ns1.nic.example. and the A is ns1.nic.  Is the 
> address record for ns1.nic. in the zone even though this might make a 
> name server refuse to load and serve the zone?
> 
> This raises the issue - what is in a zone?  I see three possible 
> (extreme) answers:
> 
> 1.) Exactly what the administrator places into the zone.
> 2.) The subset of #1 excluding typos.
> 3.) The best data that should be there.

	What the administrator places into the zone.

	You can refuse to load it but you can't split it.

	You get everything or you get nothing.  BIND operated for
	too long with best effort loading.  This, in the end, caused
	lots of problems operational problems.

	Mark

> If #1 is done perfectly right, then all three are the same.
> 
> Why not #3?  If the nameservers start editing the zone, 
> troubleshooting becomes troublesome.  From personal experience, I 
> knew of an erstwhile zone that had many, many lame delegations.  Most 
> servers for the zone also served all of the children, meaning it was 
> hard to capture the lame delegations.  But one server exposed the 
> lame delegations and that was causing operational problems. 
> Fortunately, as an operator of a slave for the zone I got a copy of 
> the zone via AXFR and was able to debug and alert the admin.
> 
> It pays to let errors become exposed.  Makes debugging easier.  Of 
> course, covering over bumps is good - if all the covering is done the 
> same way.  In an interoperable world though, nothing is always "done 
> the same way."
> 
> A comment was made at the mic in the meeting that we should think of 
> a zone "for a particular serial number."  And the zone for a 
> particular serial number is "set in stone" when the zone is 
> successfully loaded at the master server.  Not by the administrator, 
> and zones that fail to load never get to be that version.  This is 
> because only after the master loads the zone will either there be 
> NOTIFYs sent or the slaves will poll and see the incremented serial 
> number.  If any name server, especially the master, "edits" the zone 
> (that is loads a subset of what is given), the name server has taken 
> an editing pen to the administrator's work.
> 
> Why not #2?  It isn't clear if typo errors are objectively defined. 
> I haven't thought all the way through but my hunch is that trying to 
> algorithmically decide if a mistake was made is nearly impossible.
> 
> So that leaves #1, "warts and all."  In my opinion, it's the right 
> approach, but then again this is an opinion to be expressed by the 
> working group.
> 
> But let's assume for now a zone is defined as #1, and press on to the 
> issue of loading a zone (from an AXFR - as AXFR is the topic at hand).
> 
> If an AXFR will deliver to a name server the contents of a zone 
> according to the criteria of #1 above, the name server ought to do 
> some sanity checking on it.  I.e., the zone is not #3, it is not 
> ready for immediate consumption.
> 
> A name server could parse the zone and decide not to serve it due to 
> errors.  A name server has to recognize the "obscured" (or "occluded" 
> I forget the term we want to use) records.
> 
> Here's an open question.  If a name server gets a zone via AXFR 
> (presumably the name server had a reason to ask for it) and decides 
> the zone is bad and returns SERVFAIL to all queries for data in the 
> zone, will the name server still store the zone, send NOTIFYs and 
> serve it as AXFR/IXFR?
> 
> Is it possible for a name server to hold a cache of zones that failed 
> to load?  I mean, one failed load per zone configured, not a running 
> history.
> 
> Is the decision to transfer a zone different from the decision to 
> load and serve a zone?
> 
> This is meant to start an open discussion...so maybe this isn't all 
> wrapped up, but I'm seeking comments.  Eventually this will be in a 
> section about the differences between AXFR and loading.
> -- 
> -=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-
> Edward Lewis                                                +1-571-434-5468
> NeuStar
> 
> Never confuse activity with progress.  Activity pays more.
> 
> --
> to unsubscribe send a message to namedroppers-request@ops.ietf.org with
> the word 'unsubscribe' in a single line as the message text body.
> archive: <http://ops.ietf.org/lists/namedroppers/>
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Tue Aug 12 16:34:15 2008
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To: Otmar Lendl <lendl@nic.at>
Cc: Andrew Sullivan <ajs@commandprompt.com>, namedroppers@ops.ietf.org
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: DNSSEC on autopilot (was: OFFTOPIC: DNSSEC groupthink versus improving DNS) 
In-reply-to: Your message of "Tue, 12 Aug 2008 23:03:39 +0200."
             <20080812210339.GA23393@nic.at> 
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> On 2008/08/12 18:08, Andrew Sullivan <ajs@commandprompt.com> wrote:
> > On Tue, Aug 12, 2008 at 06:02:35PM +0200, Otmar Lendl wrote:
> > 
> > > I'm in brainstorming mode, so: Why can't 5011 be used by TLDs instead of
> > > extending the Registry/Registrar protocol? That change takes time
> > > and puts the Registrar into the critical path for DNSSEC rollout.
> > 
> > In at least some cases, two reasons:
> > 
> > 1.  The EPP extension for DS management has been ready for ages.  So
> > there's very little work to do there anyway.  It's in RFC 4310.  (Of
> > course, some registries aren't using EPP, so it's not relevant to them.)
> 
> It's not the protocol extension specification, which is the problem.
> It's getting the registrars to actually implement it and support it in
> their customer-facing interfaces. Bringing the registrar into the loop
> also might means legal work: T&Cs, liability questions, ...

	They are already in the loop.  They are already exposed.
	This happens the moment they attempt to change any record
	in the parent zone.  There is no difference between
	changing/adding a NS, A or AAAA records and DS records.

	You can do as much damage with any of them.

	Do the wrong thing and the zone is not visible or it is
	handed to a attacker.  DS records do not change that exposure
	in anyway.

	This is also a strength of DNSSEC.  It doesn't change the
	trust model.  The same person that is authorised to change
	the NS, A and AAAA records is also the same person that
	changes the DS records.

> > 2.  Many TLDs aren't actually allowed to talk to the party that has
> > administrative control of the domain.  In the ICANN world, for
> > instance, registries may only speak to the registrar, and not the
> > registrant.  This is admittedly a policy and not a technical reason,
> > but it's a reason anyway.
> 
> Acknowledged, but luckily that doesn't apply to .at.
> 
> /ol
> -- 
> // Otmar Lendl <lendl@nic.at>, T: +43 1 5056416 - 33, F: - 933
> // nic.at Internet Verwaltungs- und Betriebsgesellschaft m.b.H
> // http://www.nic.at/  LG Salzburg, FN 172568b, Sitz: Salzburg
> 
> --
> to unsubscribe send a message to namedroppers-request@ops.ietf.org with
> the word 'unsubscribe' in a single line as the message text body.
> archive: <http://ops.ietf.org/lists/namedroppers/>
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Wed Aug 13 03:56:01 2008
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Subject: Re: transfering vs. loading a zone
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Edward Lewis wrote:

> The issue begins with the question "what is in a zone?"  That question
> is what derailed the document a half decade ago.  The question is not
> that easy to answer.

The issue is vaguely recognized but not addressed in RFC1034 and a
solution was given 15 years ago or so in initial versions of IXFR
draft.

That is, glue As in zone information must be tagged by refferal point,
though neither zone file format nor AXFR allows to do so, which is why
I tried to fix it with IXFR.

The result was that no one else even tried to understand the issue,
which now resulted in Kaminsky's variation of ID attack with glue A.

> Here's an open question.  If a name server gets a zone via AXFR 
> (presumably the name server had a reason to ask for it) and decides the 
> zone is bad and returns SERVFAIL to all queries for data in the zone, 

Hugh? If a name server tries to receive a new version of a zone and fails,
it should continue to use an older version of the zone until it expires.

						Masataka Ohta


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From owner-namedroppers@ops.ietf.org  Wed Aug 13 04:10:49 2008
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What if you ask for a subdomain of your target and spoof a referral saying
the target name is a zone cut? This doesn't directly overwrite the cache,
but when the cached record for www.example.org expires the attacker's
nameserver will be asked for an update.

;; ->>HEADER<<- opcode: QUERY, status: NOERROR, id: 1234
;; flags: qr rd; QUERY: 1, ANSWER: 0, AUTHORITY: 1, ADDITIONAL: 1

;; QUESTION SECTION:
;345678.www.example.org.	IN	A

;; AUTHORITY SECTION:
www.example.org.	86400	IN	NS	evil.example.net.

;; ADDITIONAL SECTION:
evil.example.net.	86400	IN	A	192.0.2.53

Tony.
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SQUALLY SHOWERS. MODERATE OR GOOD.

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Hash: SHA1

Hi,

Agree with Mark, that the server that loads the zone from text file (or
whatever the first source) can refuse to send the zone through the
ecosystem.  It can admit the zone, but then keep it as written by the owner.

How to distinguish load from transfer?  After a reboot, a transferred
zone is loaded from disk.  And master or slave configuration may not be
a clue either in complicated mesh setups.

Masataka Ohta wrote:
| Edward Lewis wrote:
|> Here's an open question.  If a name server gets a zone via AXFR
|> (presumably the name server had a reason to ask for it) and decides the
|> zone is bad and returns SERVFAIL to all queries for data in the zone,
|
| Hugh? If a name server tries to receive a new version of a zone and fails,
| it should continue to use an older version of the zone until it expires.

Yes.

Best regards,
~   Wouter
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From owner-namedroppers@ops.ietf.org  Wed Aug 13 05:49:23 2008
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Date: Wed, 13 Aug 2008 08:43:53 -0400
From: Andrew Sullivan <ajs@commandprompt.com>
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Subject: Re: DNSSEC on autopilot (was: OFFTOPIC: DNSSEC groupthink versus
	improving DNS)
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References: <489B09FE.8050701@e164.org> <49451.1218124457@nsa.vix.com> <489C5202.4080405@nic.at> <20080812.164048.246546894.he@uninett.no> <48A1B41B.1060707@nic.at> <20080812164603.GA27562@commandprompt.com>
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[no hat]

On Tue, Aug 12, 2008 at 12:46:03PM -0400, Andrew Sullivan wrote:

> administrative control of the domain.  In the ICANN world, for
> instance, registries may only speak to the registrar, and not the
> registrant.  

Someone kindly reminded me that I should have been clearer about scope
here: the registries of which I'm speaking there are only the gTLDs.
Some ccTLDs have an agreement with ICANN but aren't subject to such
rules; also, of course, many (all?  I can't think of an exception at
the moment) sTLDs have a community arrangement that ensures the
registry and registrants have a direct relationship along side the
relationship between the registrant and registrar.

Sorry for any confusion,

A

-- 
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 resolvers?
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[ Moderators note: Post was moderated, either because it was posted by
   a non-subscriber, or because it was over 20K.  
   With the massive amount of spam, it is easy to miss and therefore 
   delete relevant posts by non-subscribers. 
   Please fix your subscription addresses. ]

On Mon, 11 Aug 2008, David Conrad wrote:
> 
> > Only SSL can protect you here.
> 
> As Dan Kaminsky points out: "SSL certs themselves are dependent on the  
> DNS".

Kaminsky is wrong. SSL uses DNS to obtain an IP address to connect to a
server, and then expects the server to produce a certificate, which the
client verifies. Spoofing DNS does not enable the attacker to obtain the
private key to the valid certificate.  The DNS domain information placed
in a certificate merely allows the client to determine before
verification if it got the certificate it asked for. However the wrong
or fake certificate won't verify unless there is a fault in the
Certification Authority (this happened with MS some years ago). But a
spoofed DNS name going to a wrong server results in a failure to verify
the certificate. So SSL is NOT "dependent on DNS".

Of course, if spoofed DNS sends the SSL connection to the wrong server,
a DOS attack still results since one didn't get to the correct server. 
In that sense, everything a user does is dependent on DNS. 

But it is not the case that your bank information can be stolen by this
DNS attack, as Kaminsky seems to have told the mainstream press.

		--Dean

-- 
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> But it is not the case that your bank information can be stolen by this
> DNS attack, as Kaminsky seems to have told the mainstream press.

Unless your bank used a weak cert generated on a Debian system...

Ray


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From owner-namedroppers@ops.ietf.org  Wed Aug 13 09:00:52 2008
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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers?
Date: Wed, 13 Aug 2008 11:52:14 -0400
References: <B5457C05-D2EA-4A31-94AB-84807AC62843@virtualized.org> <Pine.LNX.4.44.0808121535120.3680-100000@citation2.av8.net> <OF6BFCDCCD.B3B7FD05-ON802574A4.004C3FB5-802574A4.004C6A52@nominet.org.uk>
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On 13 Aug 2008, at 09:54, Ray.Bellis@nominet.org.uk wrote:

>> But it is not the case that your bank information can be stolen by  
>> this
>> DNS attack, as Kaminsky seems to have told the mainstream press.
>
> Unless your bank used a weak cert generated on a Debian system...

Or unless the authentication performed by the CA is easily subverted,  
leading them to sell a certificate with a to-be-spoofed common name to  
a third party.

(Requests sent on faxed letterheads; e-mail confirmations exchanged  
with the listed domain contacts; etc.)

SSL is only as good as (a) CA signing policies and (b) users  
reliability in not ignoring certificate warnings. In practice (in my  
opinion) this makes SSL protection for services quite weak, in general.


Joe


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From owner-namedroppers@ops.ietf.org  Wed Aug 13 09:11:51 2008
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At Tue, 12 Aug 2008 15:45:57 -0400 (EDT),
Dean Anderson wrote:
> On Mon, 11 Aug 2008, David Conrad wrote:
> > 
> > > Only SSL can protect you here.
> > 
> > As Dan Kaminsky points out: "SSL certs themselves are dependent on the  
> > DNS".
> 
> Kaminsky is wrong. SSL uses DNS to obtain an IP address to connect to a
> server, and then expects the server to produce a certificate, which the
> client verifies. Spoofing DNS does not enable the attacker to obtain the
> private key to the valid certificate.  The DNS domain information placed
> in a certificate merely allows the client to determine before
> verification if it got the certificate it asked for. However the wrong
> or fake certificate won't verify unless there is a fault in the
> Certification Authority (this happened with MS some years ago). But a
> spoofed DNS name going to a wrong server results in a failure to verify
> the certificate. So SSL is NOT "dependent on DNS".

Based on my brief skim of Kaminsky's presentation, I think his
argument is that because CAs often use e-mail answerback as a
certificate validation mechanism, a compromise of DNS can be used to
obtain a fake SSL/TLS certificate. Of course, there's nothing stopping
CAs from requesting more validation (in fact, I believe that's what EV
certificates already do), in which case there would not be a DNS-based
threat.

That said, it's not clear to me that the situation is significantly
better with DNSSEC.  Both certificates and signed zone signing keys
are attestations that a given public key corresponds to the owner of a
given domain name/group of names. The non-cryptographic question is
how the signer of the credential determines whether a given candidate
public key is correct. But this question is more or less the same for
DNS servers and CAs, because in both cases there is generally not a
cryptographic credential, but just an authoritative contact point,
which often reduces to an email address.

-Ekr
 

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From owner-namedroppers@ops.ietf.org  Wed Aug 13 09:18:18 2008
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At Wed, 13 Aug 2008 14:54:39 +0100,
Ray.Bellis@nominet.org.uk wrote:
> 
> > But it is not the case that your bank information can be stolen by this
> > DNS attack, as Kaminsky seems to have told the mainstream press.
> 
> Unless your bank used a weak cert generated on a Debian system...

... And you haven't installed one of the weak key blacklists.


-Ekr

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From owner-namedroppers@ops.ietf.org  Wed Aug 13 09:29:44 2008
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Date: Wed, 13 Aug 2008 09:20:17 -0700
To: "W.C.A. Wijngaards" <wouter@nlnetlabs.nl>
From: Edward Lewis <Ed.Lewis@neustar.biz>
Subject: Re: transfering vs. loading a zone
Cc: Masataka Ohta <mohta@necom830.hpcl.titech.ac.jp>,
        Edward Lewis <Ed.Lewis@neustar.biz>, namedroppers@ops.ietf.org
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Well, this is kind of what I was wondering about.

Can a name server receive a zone via AXFR, examine it and decide it's 
rotten but then turn around and send it as an AXFR server?  Would the 
server then send out NOTIFY messages as if it loaded the zone?  (Mind 
you, this is the AXFR document, but I want to know anyway.)  I 
suppose that having a rotten zone in the server would also complicate 
IXFR, huh?

Perhaps a name server should toss any rotten zones.  But, but, but...

But what if a subset of authoritative servers decide to load the zone 
with serial number 9.  The admin though sees that serial number 8 is 
the last everywhere, looks at a log of one of the rejecting machines, 
edits the zone and tries to load it as 9 again.  Now the rejecters 
will pick this up and serve it as 9, but the ones that loaded the 
previous 9 will not pick it up (as the serial number didn't 
increment).

Should a server remember the last SOA serial it saw, regardless of 
the successful loading of the one.  I.e., separation of the zone 
transfer process and loading process.

At 13:22 +0200 8/13/08, W.C.A. Wijngaards wrote:
>-----BEGIN PGP SIGNED MESSAGE-----
>Hash: SHA1
>
>Hi,
>
>Agree with Mark, that the server that loads the zone from text file (or
>whatever the first source) can refuse to send the zone through the
>ecosystem.  It can admit the zone, but then keep it as written by the owner.
>
>How to distinguish load from transfer?  After a reboot, a transferred
>zone is loaded from disk.  And master or slave configuration may not be
>a clue either in complicated mesh setups.
>
>Masataka Ohta wrote:
>| Edward Lewis wrote:
>|> Here's an open question.  If a name server gets a zone via AXFR
>|> (presumably the name server had a reason to ask for it) and decides the
>|> zone is bad and returns SERVFAIL to all queries for data in the zone,
>|
>| Hugh? If a name server tries to receive a new version of a zone and fails,
>| it should continue to use an older version of the zone until it expires.
>
>Yes.
>
>Best regards,
>~   Wouter
>-----BEGIN PGP SIGNATURE-----
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Edward Lewis                                                +1-571-434-5468
NeuStar

Never confuse activity with progress.  Activity pays more.

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Date: Wed, 13 Aug 2008 16:22:20 +0000
From: bmanning@vacation.karoshi.com
To: Joe Abley <jabley@ca.afilias.info>
Cc: Ray.Bellis@nominet.org.uk, Namedroppers WG <namedroppers@ops.ietf.org>
Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers?
Message-ID: <20080813162220.GA1285@vacation.karoshi.com.>
References: <B5457C05-D2EA-4A31-94AB-84807AC62843@virtualized.org> <Pine.LNX.4.44.0808121535120.3680-100000@citation2.av8.net> <OF6BFCDCCD.B3B7FD05-ON802574A4.004C3FB5-802574A4.004C6A52@nominet.org.uk> <764E89A0-32D2-4555-B61C-C8B7D88EB9E1@ca.afilias.info>
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On Wed, Aug 13, 2008 at 11:52:14AM -0400, Joe Abley wrote:
> 
> On 13 Aug 2008, at 09:54, Ray.Bellis@nominet.org.uk wrote:
> 
> >>But it is not the case that your bank information can be stolen by  
> >>this
> >>DNS attack, as Kaminsky seems to have told the mainstream press.
> >
> >Unless your bank used a weak cert generated on a Debian system...
> 
> Or unless the authentication performed by the CA is easily subverted,  
> leading them to sell a certificate with a to-be-spoofed common name to  
> a third party.
> 
> (Requests sent on faxed letterheads; e-mail confirmations exchanged  
> with the listed domain contacts; etc.)
> 
> SSL is only as good as (a) CA signing policies and (b) users  
> reliability in not ignoring certificate warnings. In practice (in my  
> opinion) this makes SSL protection for services quite weak, in general.
> 
> Joe


do i have the dance steps right?

	trap a query/response pair

	forge the reply - stuff the additional section w/ self-executing code to
		dump a self-signed cert to a "mimic" bank site into the local 
		browser cache

	stuff the DNS cache with a "mismatched" name -> address pair, where the
		address is to the "mimic" site.

	the browser is none the wiser, SSL is happy.

looks like the  walz of deception to me.

--bill

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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable
	resolvers?
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On Wed, Aug 13, 2008 at 11:52:14AM -0400, Joe Abley wrote:
> On 13 Aug 2008, at 09:54, Ray.Bellis@nominet.org.uk wrote:
>>> But it is not the case that your bank information can be stolen by this
>>> DNS attack, as Kaminsky seems to have told the mainstream press.
>>
>> Unless your bank used a weak cert generated on a Debian system...
>
> Or unless the authentication performed by the CA is easily subverted, 
> leading them to sell a certificate with a to-be-spoofed common name to a 
> third party.

Or even Kaminsky-subverting http://www.bank.com/ to point to a host
which produces a redirect to https://www.bankfoo.com/, which is under
the attacker's full control.

-- 
Ash bugud-gul durbatuluk agh burzum-ishi krimpatul.
Why settle for the lesser evil?	 https://secure.isc.org/store/t-shirt/
-- 
David W. Hankins	"If you don't do it right the first time,
Software Engineer		     you'll just have to do it again."
Internet Systems Consortium, Inc.		-- Jack T. Hankins

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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers?
References: <B5457C05-D2EA-4A31-94AB-84807AC62843@virtualized.org>	<Pine.LNX.4.44.0808121535120.3680-100000@citation2.av8.net>	<OF6BFCDCCD.B3B7FD05-ON802574A4.004C3FB5-802574A4.004C6A52@nominet.org.uk> <20080813162304.9AA7250846@romeo.rtfm.com>
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Eric Rescorla wrote:
> At Wed, 13 Aug 2008 14:54:39 +0100,
> Ray.Bellis@nominet.org.uk wrote:
>   
>>> But it is not the case that your bank information can be stolen by this
>>> DNS attack, as Kaminsky seems to have told the mainstream press.
>>>       
>> Unless your bank used a weak cert generated on a Debian system...
>>     
>
> ... And you haven't installed one of the weak key blacklists.
>   

The issue here isn't one of us, it's the typical banking customer.  Have 
they installed one of the weak key blacklists?  I think not.

-Jim


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To: bmanning@vacation.karoshi.com
Cc: Joe Abley <jabley@ca.afilias.info>,
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At Wed, 13 Aug 2008 16:22:20 +0000,
bmanning@vacation.karoshi.com wrote:
> 
> On Wed, Aug 13, 2008 at 11:52:14AM -0400, Joe Abley wrote:
> > 
> > On 13 Aug 2008, at 09:54, Ray.Bellis@nominet.org.uk wrote:
> > 
> > >>But it is not the case that your bank information can be stolen by  
> > >>this
> > >>DNS attack, as Kaminsky seems to have told the mainstream press.
> > >
> > >Unless your bank used a weak cert generated on a Debian system...
> > 
> > Or unless the authentication performed by the CA is easily subverted,  
> > leading them to sell a certificate with a to-be-spoofed common name to  
> > a third party.
> > 
> > (Requests sent on faxed letterheads; e-mail confirmations exchanged  
> > with the listed domain contacts; etc.)
> > 
> > SSL is only as good as (a) CA signing policies and (b) users  
> > reliability in not ignoring certificate warnings. In practice (in my  
> > opinion) this makes SSL protection for services quite weak, in general.
> > 
> > Joe
> 
> 
> do i have the dance steps right?
> 
> 	trap a query/response pair
> 
> 	forge the reply - stuff the additional section w/ self-executing code to
> 		dump a self-signed cert to a "mimic" bank site into the local 
> 		browser cache

This is the step I got lost at. You're assuming that there is some bug in the
browser that will allow a malicious DNS response to inject information
into the browser certificate cache? It's certainly possible that that's
true, but if so, then you've most likely got a generic remote exploit
for the browser, so why bother with any fanciness about trapping queries
and responses, SSL, etc get the user to dereference *your* domain name (remember
that the premise here is that the attacker can get the user to dereference
domain names of his choice) stuff the attack payload in the response
and subvert the user's computer directly?


> 	stuff the DNS cache with a "mismatched" name -> address pair, where the
> 		address is to the "mimic" site.
> 
> 	the browser is none the wiser, SSL is happy.
> 
> looks like the  walz of deception to me.

Again, why other with this stuff? At this point you control the user's computer
and can simply passively tap all his communications.

-Ekr

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Date: Wed, 13 Aug 2008 10:18:16 -0700
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	Namedroppers WG <namedroppers@ops.ietf.org>
Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers?
In-Reply-To: <764E89A0-32D2-4555-B61C-C8B7D88EB9E1@ca.afilias.info>
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At Wed, 13 Aug 2008 11:52:14 -0400,
Joe Abley wrote:
> 
> 
> On 13 Aug 2008, at 09:54, Ray.Bellis@nominet.org.uk wrote:
> 
> >> But it is not the case that your bank information can be stolen by  
> >> this
> >> DNS attack, as Kaminsky seems to have told the mainstream press.
> >
> > Unless your bank used a weak cert generated on a Debian system...
> 
> Or unless the authentication performed by the CA is easily subverted,  
> leading them to sell a certificate with a to-be-spoofed common name to  
> a third party.
> 
> (Requests sent on faxed letterheads; e-mail confirmations exchanged  
> with the listed domain contacts; etc.)
> 
> SSL is only as good as (a) CA signing policies and (b) users  
> reliability in not ignoring certificate warnings. In practice (in my  
> opinion) this makes SSL protection for services quite weak, in general.

As I should have stated earlier, I'm not offering a general defense of
SSL certificates or PKI practices in general. However, exactly these
same issues apply to decisions made about DNS domain transfers/
information modification, key signing, etc.

The problem here is not PKI or DNSSEC but that we have no good
mechanisms in the generic case for determining whether a given
individual is authorized to control a given domain. This makes any
cryptographic authentication of domain name ownership problematic.

-Ekr


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From owner-namedroppers@ops.ietf.org  Wed Aug 13 10:24:43 2008
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Date: Wed, 13 Aug 2008 10:31:40 -0700
From: Eric Rescorla <ekr@networkresonance.com>
To: Jim Fenton <fenton@cisco.com>
Cc: Eric Rescorla <ekr@networkresonance.com>,
	Ray.Bellis@nominet.org.uk,
	Namedroppers WG <namedroppers@ops.ietf.org>
Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers?
In-Reply-To: <48A314C1.7060907@cisco.com>
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At Wed, 13 Aug 2008 10:07:13 -0700,
Jim Fenton wrote:
>=20
> Eric Rescorla wrote:
> > At Wed, 13 Aug 2008 14:54:39 +0100,
> > Ray.Bellis@nominet.org.uk wrote:
> >  =20
> >>> But it is not the case that your bank information can be stolen by th=
is
> >>> DNS attack, as Kaminsky seems to have told the mainstream press.
> >>>      =20
> >> Unless your bank used a weak cert generated on a Debian system...
> >>    =20
> >
> > ... And you haven't installed one of the weak key blacklists.
> >  =20
>=20
> The issue here isn't one of us, it's the typical banking customer.  Have =

> they installed one of the weak key blacklists?  I think not.

Yes, I agree that it would be nice if the browsers shipped out of the
box with blacklisting.=20

Of course, that depends on the users running the latest version of
the browser (see [FDOM08]), but if they're not then presumably
they're open to all sorts of non-TLS remote exploits, so why is this
one special?

-Ekr

[FDOM08] S. Frei, T. D=FCbendorfer, G. Ollmann, M. May, "Understanding the =
Web
browser threat: Examination of vulnerable online Web browser populations
and the "insecurity iceberg"", Defcon 2008, August 2008.

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From owner-namedroppers@ops.ietf.org  Wed Aug 13 10:24:52 2008
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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers?
Date: Wed, 13 Aug 2008 10:19:00 -0700
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On Aug 12, 2008, at 12:45 PM, Dean Anderson wrote:
> But it is not the case that your bank information can be stolen by  
> this
> DNS attack, as Kaminsky seems to have told the mainstream press.

You are right that SSL would protect the user.   However, the Kaminsky  
vulnerability provides an opportunity for a downgrade attack.   If the  
attacker presents a self-signed cert, some percentage of users will  
accept it, thus accepting the security downgrade.   For those users,  
the fact that SSL would protect them doesn't help.   If we can stop  
the Kaminsky attack, we can prevent this particular downgrade attack.

Security is not just about secure protocols.   You have to take into  
account what the user will do as well.   A thousand-dollar safe is no  
use you don't lock it.


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From owner-namedroppers@ops.ietf.org  Wed Aug 13 10:32:08 2008
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CC: "bmanning@vacation.karoshi.com" <bmanning@vacation.karoshi.com>, Joe Abley
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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers?
Date: Wed, 13 Aug 2008 10:27:14 -0700
References: <B5457C05-D2EA-4A31-94AB-84807AC62843@virtualized.org> <Pine.LNX.4.44.0808121535120.3680-100000@citation2.av8.net> <OF6BFCDCCD.B3B7FD05-ON802574A4.004C3FB5-802574A4.004C6A52@nominet.org.uk> <764E89A0-32D2-4555-B61C-C8B7D88EB9E1@ca.afilias.info> <20080813172224.D89DC50846@romeo.rtfm.com>
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Eric, one other thing to bear in mind with banks is that the typical  
user goes to http://www.bank.com and types in their password in the  
login form presented to them.   All I (the attacker) have to do to get  
their password is to arrange for the form with which they are  
presented to submit the password to an http:// URL instead of the  
bank's HTTPS:// URL.   SSL doesn't happen, so the user is not told  
about the invalid cert.   And chances are they've disabled the  
"insecure form" warning, because it pops up too often in cases where  
it doesn't matter.

The attacker can then tunnel the rest of the session, presenting the  
user with the illusion that they have in fact completed a transaction  
with the bank, leaving them no wiser to the fact that their login  
information has been compromised.

This will work even if the bank has a policy of presenting password  
forms only on SSL pages, because the average user won't know this, and  
thus won't be suspicious if they are offered a login on a non-https://  
page.

So the dance that's involved in phishing the user is really a lot  
simpler than you think, and the value of subverting the DNS is thus a  
lot higher.


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Ray.Bellis@nominet.org.uk wrote:
>> But it is not the case that your bank information can be stolen by this
>> DNS attack, as Kaminsky seems to have told the mainstream press.
> 
> Unless your bank used a weak cert generated on a Debian system...

US banks are notorious for not using https URIs for the initial form
where customers log in to web banking, someone was doing up a name and
shame list on banks a while back over this.

-- 

Best regards,
 Duane

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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers?
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> Or even Kaminsky-subverting http://www.bank.com/ to point to a host
> which produces a redirect to https://www.bankfoo.com/, which is under
> the attacker's full control.

no real reason to s/bank/bankfoo/ in that example.  once you've got the A RR
for www.bank.com you can just not redirect folks to https:.  (their bookmark
is likely to be for the http: site, as will their search engine exit.)  or if
the attacker wants to get CRAZY they can redirect to https: quite safely since
the majority of endusers will just click "OK" on the resulting X.509 warning,
without reading it or understanding it.

kaminsky's plan to get a key issued by polluting the caching server of a CA so
that one can successfully emulate the desired common-name attribute is harder
work than needs doing, and so, i predict the criminals will take an easier way.

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From owner-namedroppers@ops.ietf.org  Wed Aug 13 11:02:30 2008
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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers?
Date: Wed, 13 Aug 2008 10:57:22 -0700
References: <B5457C05-D2EA-4A31-94AB-84807AC62843@virtualized.org> <Pine.LNX.4.44.0808121535120.3680-100000@citation2.av8.net> <20080813161754.6E16850846@romeo.rtfm.com>
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On Aug 13, 2008, at 9:17 AM, Eric Rescorla wrote:
> At Tue, 12 Aug 2008 15:45:57 -0400 (EDT),
>>>> Only SSL can protect you here.
>>> As Dan Kaminsky points out: "SSL certs themselves are dependent on  
>>> the
>>> DNS".
>> Kaminsky is wrong.
> Based on my brief skim of Kaminsky's presentation, I think his
> argument is that because CAs often use e-mail answerback as a
> certificate validation mechanism, a compromise of DNS can be used to
> obtain a fake SSL/TLS certificate.

That is (as I understand) part of it.

> Of course, there's nothing stopping
> CAs from requesting more validation (in fact, I believe that's what EV
> certificates already do), in which case there would not be a DNS-based
> threat.

Right.  And if the CA uses VOIP that does a DNS lookup, or if the  
databases the CA uses are reached via DNS, or if the CA uses software  
that does self-updates after looking up the 'phone home' server via  
DNS, or ....

I believe what Dan was pointing out is the DNS is an underlying  
infrastructure which all sorts of other infrastructure relies upon and  
if you can crack the DNS infrastructure, lots of other stuff becomes  
much more "interesting" (in the Ebola virus sense of 'interesting'),  
sometimes in ways that aren't necessarily obvious.

Regards,
-drc


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From owner-namedroppers@ops.ietf.org  Wed Aug 13 11:15:13 2008
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Date: Wed, 13 Aug 2008 19:09:52 +0100
From: Alex Bligh <alex@alex.org.uk>
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To: Paul Vixie <vixie@isc.org>, "David W. Hankins" <David_Hankins@isc.org>
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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable
 resolvers?
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--On 13 August 2008 17:35:01 +0000 Paul Vixie <vixie@isc.org> wrote:

>> Or even Kaminsky-subverting http://www.bank.com/ to point to a host
>> which produces a redirect to https://www.bankfoo.com/, which is under
>> the attacker's full control.
>
> no real reason to s/bank/bankfoo/ in that example.  once you've got the A
> RR for www.bank.com you can just not redirect folks to https:.

Perhaps there is no real reason but all 4 of the online banking services
I use do this.

Alex

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From owner-namedroppers@ops.ietf.org  Wed Aug 13 16:23:00 2008
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To: Edward Lewis <Ed.Lewis@neustar.biz>
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: transfering vs. loading a zone 
In-reply-to: Your message of "Wed, 13 Aug 2008 09:20:17 MST."
             <a06240800c4c8b89dde7a@[0.0.0.0]> 
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> Well, this is kind of what I was wondering about.
> 
> Can a name server receive a zone via AXFR, examine it and decide it's 
> rotten but then turn around and send it as an AXFR server?  Would the 
> server then send out NOTIFY messages as if it loaded the zone?  (Mind 
> you, this is the AXFR document, but I want to know anyway.)  I 
> suppose that having a rotten zone in the server would also complicate 
> IXFR, huh?

	Ed, if the zone is deemed rotten then the SOA queries will
	not be answered and the downstream slave will not attempt
	to AXFR from the upstream slave.

	IXFR should conceptually be the same.  The rotten SOA should
	not be visible to the IXFR process.

	All or nothing.  Anything else is a problem waiting to
	happen.
 
> Perhaps a name server should toss any rotten zones.  But, but, but...
> 
> But what if a subset of authoritative servers decide to load the zone 
> with serial number 9.  The admin though sees that serial number 8 is 
> the last everywhere, looks at a log of one of the rejecting machines, 
> edits the zone and tries to load it as 9 again.  Now the rejecters 
> will pick this up and serve it as 9, but the ones that loaded the 
> previous 9 will not pick it up (as the serial number didn't 
> increment).

	The administrator failed to manage the serial number properly,
	the results are outside the protocol because the administator
	failed to follow the protocol.

> Should a server remember the last SOA serial it saw, regardless of 
> the successful loading of the one.  I.e., separation of the zone 
> transfer process and loading process.

	There is no need for the slave to remember.  If the
	administrator follows the protocol it is not required.
 
	Mark
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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To: Eric Rescorla <ekr@networkresonance.com>
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers? 
In-reply-to: Your message of "Wed, 13 Aug 2008 10:18:16 MST."
             <20080813171816.D7B3C50846@romeo.rtfm.com> 
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> The problem here is not PKI or DNSSEC but that we have no good
> mechanisms in the generic case for determining whether a given
> individual is authorized to control a given domain. This makes any
> cryptographic authentication of domain name ownership problematic.

	Most zones are created when they are bought.  The buyer
	specifies the NS, DS and glue records as part of that
	transaction.  The credentials for future transactions are
	established as part of that initial transaction.

	Now when zones are sold there are issues but those issues
	exist independent of whether DNSSEC is in use or not.

	If you are authorised to update the delegation information
	in the parent then you should be authorised to change the
	DS records in the parent as they are just part of the
	delegation.  Changes to NS, A, AAAA and DS records as part
	of the delegation are equally dangerous as each other.

	There is no need to make the parent / child trust relationship
	more complicated with DNSSEC than it is without DNSSEC.

	Mark
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Wed Aug 13 18:23:12 2008
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Date: Wed, 13 Aug 2008 18:16:25 -0700
From: Eric Rescorla <ekr@networkresonance.com>
To: Mark Andrews <Mark_Andrews@isc.org>
Cc: Eric Rescorla <ekr@networkresonance.com>,
	Joe Abley <jabley@ca.afilias.info>,
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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers? 
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At Thu, 14 Aug 2008 10:43:46 +1000,
Mark Andrews wrote:
> 
> 
> > The problem here is not PKI or DNSSEC but that we have no good
> > mechanisms in the generic case for determining whether a given
> > individual is authorized to control a given domain. This makes any
> > cryptographic authentication of domain name ownership problematic.
> 
> 	Most zones are created when they are bought.  The buyer
> 	specifies the NS, DS and glue records as part of that
> 	transaction.  The credentials for future transactions are
> 	established as part of that initial transaction.
> 
> 	Now when zones are sold there are issues but those issues
> 	exist independent of whether DNSSEC is in use or not.
> 
> 	If you are authorised to update the delegation information
> 	in the parent then you should be authorised to change the
> 	DS records in the parent as they are just part of the
> 	delegation.  Changes to NS, A, AAAA and DS records as part
> 	of the delegation are equally dangerous as each other.
> 
> 	There is no need to make the parent / child trust relationship
> 	more complicated with DNSSEC than it is without DNSSEC.

Yes, I agree with that. But in many of these cases, the credentials
are "here's the email address to contact the technical contact with".
This is of course just as problematic as e-mail answerback for 
certificate authorites. 

And to the extent to which the registrars/registries have a
DNS-independent way of validating the domain owners, the CAs 
(who in at least some cases are the same people!) could
presumably leverage that to determine whether to issue
the certs.

-Ekr


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From owner-namedroppers@ops.ietf.org  Wed Aug 13 21:38:03 2008
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Cc: Joe Abley <jabley@ca.afilias.info>, Ray.Bellis@nominet.org.uk,
        Namedroppers WG <namedroppers@ops.ietf.org>
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers? 
In-reply-to: Your message of "Wed, 13 Aug 2008 18:16:25 MST."
             <20080814011626.2DAE05369E9@kilo.rtfm.com> 
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> At Thu, 14 Aug 2008 10:43:46 +1000,
> Mark Andrews wrote:
> > 
> > 
> > > The problem here is not PKI or DNSSEC but that we have no good
> > > mechanisms in the generic case for determining whether a given
> > > individual is authorized to control a given domain. This makes any
> > > cryptographic authentication of domain name ownership problematic.
> > 
> > 	Most zones are created when they are bought.  The buyer
> > 	specifies the NS, DS and glue records as part of that
> > 	transaction.  The credentials for future transactions are
> > 	established as part of that initial transaction.
> > 
> > 	Now when zones are sold there are issues but those issues
> > 	exist independent of whether DNSSEC is in use or not.
> > 
> > 	If you are authorised to update the delegation information
> > 	in the parent then you should be authorised to change the
> > 	DS records in the parent as they are just part of the
> > 	delegation.  Changes to NS, A, AAAA and DS records as part
> > 	of the delegation are equally dangerous as each other.
> > 
> > 	There is no need to make the parent / child trust relationship
> > 	more complicated with DNSSEC than it is without DNSSEC.
> 
> Yes, I agree with that. But in many of these cases, the credentials
> are "here's the email address to contact the technical contact with".
> This is of course just as problematic as e-mail answerback for 
> certificate authorites. 

	And how does this change with DNSSEC?  DNSSEC doesn't
	magically make this any more or less important / difficult.

	This is NOT a DNSSEC issue.  It is a delegation management
	issue and DNSSEC does NOT change the level of care required
	when managing a delegation.  All DNSSEC changes is whether
	a DS record is recorded at the delegation or not.

	Labeling this a DNSSEC deployment issue is doing DNSSEC a
	dis-service.

	What would help would be for ICANN to list which registrars
	support DS and/or AAAA records as part of normal operations
	and which ones don't.  By normal operations I mean that you
	don't have to send special email to get the records added.

	At the moment it's hard to find a registrar which supports
	AAAA and/or DS records.

> And to the extent to which the registrars/registries have a
> DNS-independent way of validating the domain owners, the CAs 
> (who in at least some cases are the same people!) could
> presumably leverage that to determine whether to issue
> the certs.
> 
> -Ekr
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Wed Aug 13 22:19:34 2008
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To: "W.C.A. Wijngaards" <wouter@nlnetlabs.nl>
CC: Edward Lewis <Ed.Lewis@neustar.biz>,  namedroppers@ops.ietf.org
Subject: Re: transfering vs. loading a zone
References: <a06240800c4c752b74d81@[192.168.50.50]> <48A2BB7D.90408@necom830.hpcl.titech.ac.jp> <48A2C3E9.9070000@nlnetlabs.nl>
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W.C.A. Wijngaards wrote:

> Agree with Mark, that the server that loads the zone from text file (or
> whatever the first source) can refuse to send the zone through the
> ecosystem.  It can admit the zone, but then keep it as written by the 
> owner.

With AXFR/IXFR, that is an issue only with the primary nameservers.
Though RFC1034 does not disallow zone transfer with text files transferred
by ftp or e-mail, nameservers receiving text zone should be considered
the primary with regrad to AXFR/IXFR discussion.

The problem here, however, is that zone contents recognized valid
by the primary nameserver may be recognized invalid by secondary
nameservers.

Such inconsistencies are often caused by violent application of the
concept of "bailiwick" to glue As.

> | Hugh? If a name server tries to receive a new version of a zone and 
> fails,
> | it should continue to use an older version of the zone until it expires.
> 
> Yes.

And, we hope zone administrators take care of inconsistencies between
nameservers before or, in practice hopefully, immediately after the
zone expiration.

							Masataka Ohta



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From owner-namedroppers@ops.ietf.org  Wed Aug 13 22:40:37 2008
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Subject: Re: How do we get the whole world to upgrade to DNSSEC capable resolvers?
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Mark Andrews wrote:

> 	What would help would be for ICANN to list which registrars
> 	support DS and/or AAAA records as part of normal operations

Can't help you with DS records, but as for AAAA records:

http://www.sixxs.net/faq/dns/?faq=ipv6glue

-- 

Best regards,
 Duane

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From owner-namedroppers@ops.ietf.org  Thu Aug 14 09:49:36 2008
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To: namedroppers@ops.ietf.org
From: =?iso-8859-1?Q?=D3lafur?= =?iso-8859-1?Q?_Gu=F0mundsson?= /DNSEXT 
 chair <ogud@ogud.com>
Subject: Re: Working Group Last Call for
  draft-ietf-dnsext-rfc2672bis-dname-14
In-Reply-To: <20080731173241.GB93159@commandprompt.com>
References: <20080731173241.GB93159@commandprompt.com>
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I know everyone is preoccupied with other thoughts for the last few weeks.
Please page this draft back into your brain and send comments or at least that
you have read it and/or support its advance.

         Thanks
         Olafur


At 13:32 31/07/2008, Andrew Sullivan wrote:
>Dear colleagues,
>
>This message starts a four week working group last call for "Update to
>DNAME Redirection in the DNS".  The latest draft, and the history of
>the document, can be found at
><http://tools.ietf.org/wg/dnsext/draft-ietf-dnsext-rfc2672bis-dname/>.
>If approved, the document will obsolete RFC 2672.  If approved, the
>document will update RFC 3363 and RFC 4294.
>
>Please read the document carefully.  Please send any remarks you have
>about the draft to the working group mailing list.
>
>The document process rules for this working group require that five
>working group members state that they have read the document, and that
>there be consensus that the document be published as a standards track
>document with a target status of Proposed Standard.
>
>The last call ends at 2008-08-28 17:00 EDT.
>
>Best regards,
>
>Andrew (for the chairs)
>
>--
>Andrew Sullivan
>ajs@commandprompt.com
>+1 503 667 4564 x104
>http://www.commandprompt.com/
>
>--
>to unsubscribe send a message to namedroppers-request@ops.ietf.org with
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From owner-namedroppers@ops.ietf.org  Thu Aug 14 14:09:07 2008
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Dean Anderson wrote:
> The assertion of personal attacks is a lie and a deception of the 
> working group.
>
>
>   

[ Personal attack on Andrew Sullivan elided for brevity.  Any future 
claim by Mr. Anderson in the regard, should be taken as patently false. ]

I can personally attest to both the integrity of Andrew Sullivan, and to 
the fact that everything said about him was false.

I can't recall - is it libel or slander, when someone maligns someone 
else in writing in a malicious manner?

> This abuse has to stop.
>
> 		--Dean
>   
>

Yes, you are right on this point.

Please stop abusing people on IETF mailing lists.

Brian

P.S. NO ONE ELSE FEED THE TROLL, PLEASE.

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--NextPart

A New Internet-Draft is available from the on-line Internet-Drafts directories.
This draft is a work item of the DNS Extensions Working Group of the IETF.


	Title           : Measures for making DNS more resilient against forged answers
	Author(s)       : B. Hubert, R. Mook
	Filename        : draft-ietf-dnsext-forgery-resilience-07.txt
	Pages           : 25
	Date            : 2008-08-14

The current Internet climate poses serious threats to the Domain Name
System.  In the interim period before the DNS protocol can be secured
more fully, measures can already be taken to harden the DNS to make
'spoofing' a recursing nameserver many orders of magnitude harder.

Even a cryptographically secured DNS benefits from having the ability
to discard bogus responses quickly, as this potentially saves large
amounts of computation.

By describing certain behaviour that has previously not been
standardised, this document sets out how to make the DNS more
resilient against accepting incorrect responses.  This document
updates RFC 1034.

A URL for this Internet-Draft is:
http://www.ietf.org/internet-drafts/draft-ietf-dnsext-forgery-resilience-07.txt

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From owner-namedroppers@ops.ietf.org  Thu Aug 14 15:09:29 2008
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Date: Fri, 15 Aug 2008 00:04:16 +0200
From: bert hubert <bert.hubert@netherlabs.nl>
To: namedroppers@ops.ietf.org
Subject: Re: I-D Action:draft-ietf-dnsext-forgery-resilience-07.txt
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On Thu, Aug 14, 2008 at 02:45:01PM -0700, Internet-Drafts@ietf.org wrote:
> A New Internet-Draft is available from the on-line Internet-Drafts directories.
> This draft is a work item of the DNS Extensions Working Group of the IETF.

The (almost) full diff between -06 and -07 can be found on 
http://adsl-xs4all.ds9a.nl/cgi-bin/resilience.fcgi/changeset/35

The remainder is s/July/August/ and s/-06/-07/.

All changes are non-normative and solely descriptive.

	Bert

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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From owner-namedroppers@ops.ietf.org  Thu Aug 14 15:48:15 2008
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Date: Thu, 14 Aug 2008 18:43:26 -0400
From: Andrew Sullivan <ajs@commandprompt.com>
To: namedroppers@ops.ietf.org
Subject: Working Group Last Call for   draft-ietf-dnsext-dnssec-rsasha256-05
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Dear colleagues,

Although it is one week later than we indicated at the Dublin meeting,
this message starts a four week working group last call for "Use of
SHA-2 algorithms with RSA in DNSKEY and RRSIG Resource Records for
DNSSEC".  The latest draft, and the history of the document, can be
found at
<http://tools.ietf.org/wg/dnsext/draft-ietf-dnsext-dnssec-rsasha256/>.

The docment is intended for the standards track, and if adopted will
become a Proposed Standard.

Please read the document carefully.  Please send any remarks you have
about the draft to the working group mailing list.  

The document process rules for this working group require that they
have read the document, and that there be consensus that the document
be published as a standards track document, with a target status of
Proposed Standard.

The last call ends at 2008-09-11 17:00 EDT.

Best regards,

Andrew (for the chairs)

-- 
Andrew Sullivan
ajs@commandprompt.com
+1 503 667 4564 x104
http://www.commandprompt.com/

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From owner-namedroppers@ops.ietf.org  Thu Aug 14 17:48:48 2008
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Date: Thu, 14 Aug 2008 17:42:41 -0700
To: namedroppers@ops.ietf.org
From: Paul Hoffman <paul.hoffman@vpnc.org>
Subject: Re: Working Group Last Call for  
 draft-ietf-dnsext-dnssec-rsasha256-05
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Two minor issues with references:

- There is no reason to have the [SCHNEIER-1996] reference: pointing 
directly to RFC 3447 for "familiarity with RSA" is sufficient.

- The reference to RFC 4641 for determining key size should be 
removed. The problems with the crypto in RFC 4641 is being discussed 
in the DNSOPS WG, NIST SP 800-57 is still an excellent reference on 
key sizes.

--Paul Hoffman, Director
--VPN Consortium

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From owner-namedroppers@ops.ietf.org  Thu Aug 14 21:04:00 2008
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Date: Thu, 14 Aug 2008 23:56:36 -0400
From: Andrew Sullivan <ajs@commandprompt.com>
To: Dean Anderson <dean@av8.com>, namedroppers@ops.ietf.org
Subject: A note of apology (Was: Kaminsky, Cache Poisoning, and Censorship)
Message-ID: <20080815035635.GI63791@commandprompt.com>
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Dear colleagues,

Dean Anderson has brought an error to my attention:

On Thu, Aug 14, 2008 at 04:31:52PM -0400, Dean Anderson wrote:
> 
> > [ Moderators note: Post was moderated, either because it was posted by
> >    a non-subscriber, or because it was over 20K.
> >    With the massive amount of spam, it is easy to miss and therefore
> >    delete relevant posts by non-subscribers.
> >    Please fix your subscription addresses. ]
>  
> The moderators note is false, and deceives the Working Group. I am a
> subscriber, and the post was not over 20K.

I wish to apologise to the members of the Working Group, and to Mr
Anderson, for my error.  Mr Anderson, as many of you may be aware, had
his posting privileges revoked [1].  Because of that, Mr Anderson's
post was caught in the same trap as non-subscribers' mail.  When I
approved it, I used an incorrect mechanism.  That mechanism added the
"Moderator's note" text you see quoted by Mr Anderson.

The inserted text is therefore my fault, and I wish to correct the
error.  Mr Anderson's post was not moderated because of being posted
by a non-subscriber, or because of its size.  It was moderated
because, while Mr Anderson is a subscriber to the mailing list, he is
not automatically allowed to post.  I should have used a different
mechanism to approve his post (one that would not have added only that
text).

I regret the error.  Olafur and I are currently reviewing mailing list
administration, but this particular mistake is entirely mine.

Best regards,

Andrew

[1] http://ops.ietf.org/lists/namedroppers/namedroppers.2008/msg00149.html

-- 
Andrew Sullivan
ajs@commandprompt.com
+1 503 667 4564 x104
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From owner-namedroppers@ops.ietf.org  Fri Aug 15 06:38:54 2008
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Date: Fri, 15 Aug 2008 00:01:42 -0400 (EDT)
From: Dean Anderson <dean@av8.com>
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To: Brian Dickson <briand@ca.afilias.info>
cc: Joe Abley <jabley@ca.afilias.info>,
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Subject: Re: Kaminsky, Cache Poisoning, and Censorship
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[ Note: Post was moderated. ] 

On Thu, 14 Aug 2008, Brian Dickson wrote:

> Dean Anderson wrote:
> > The assertion of personal attacks is a lie and a deception of the 
> > working group.


> I can personally attest to both the integrity of Andrew Sullivan, and to 
> the fact that everything said about him was false.

What personal knowledge do you have of the facts?  If you have no
personal knowledge of the facts, you can't make any true statement as to
the facts.  If you have direct personal knowledge and were involved
personally, please let me know.


> I can't recall - is it libel or slander, when someone maligns someone 
> else in writing in a malicious manner?

Its libel.  False reports of misconduct are libel.

What I said was true, and what Andrew said about me was false.

		--Dean

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From owner-namedroppers@ops.ietf.org  Fri Aug 15 06:38:55 2008
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From: Dean Anderson <dean@av8.com>
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To: Ben Laurie <ben@links.org>, Alex Bligh <alex@alex.org.uk>,
        David Conrad <drc@virtualized.org>,
        bert hubert <bert.hubert@netherlabs.nl>,
        Ted Lemon <Ted.Lemon@nominum.com>, Mark Andrews <Mark_Andrews@isc.org>,
        <bmanning@karoshi.com>, Brian Dickson <briand@ca.afilias.info>,
        Joe Abley <jabley@ca.afilias.info>, Jelte Jansen <jelte@NLnetLabs.nl>,
        Andrew Sullivan <ajs@commandprompt.com>,
        Roy Arends <roy@nominet.org.uk>, <bmanning@vacation.karoshi.com>,
        Stephane Bortzmeyer <bortzmeyer@nic.fr>,
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        Michael StJohns <mstjohns@comcast.net>, <Ray.Bellis@nominet.org.uk>,
        Eric Rescorla <ekr@networkresonance.com>,
        "David W. Hankins" <David_Hankins@isc.org>,
        Duane at e164 dot org <duane@e164.org>, Jim Fenton <fenton@cisco.com>,
        Paul Vixie <vixie@isc.org>,
        Masataka Ohta <mohta@necom830.hpcl.titech.ac.jp>
cc: DNSEXT WG <namedroppers@ops.ietf.org>, <iesg@ietf.org>
Subject: Kaminsky, Cache Poisoning, and Censorship
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[ Note: Post was moderated. ] 


> [ Moderators note: Post was moderated, either because it was posted by
>    a non-subscriber, or because it was over 20K.
>    With the massive amount of spam, it is easy to miss and therefore
>    delete relevant posts by non-subscribers.
>    Please fix your subscription addresses. ]
 
The moderators note is false, and deceives the Working Group. I am a
subscriber, and the post was not over 20K.
  
The Chairs have chosen to censor messages which are relevant to WG
business, but that are not exclusively technical.  The type of messages
they have said they will censor includes messages about RFC3979
compliance, messages about financial considerations for drafts, and
messages concerning the integrity of the IETF process as described by
RFC2026 section 6.5.1. In practice, they have blocked messages that
merely oppose the unsubstantiated assertions of the BIND Cartel (ISC,
Nomimum, UltraDNS, and Centergate Research)

See http://www.av8.net/IETF-watch/DNSEXT/Management.html

The assertion of personal attacks is a lie and a deception of the 
working group.

In 2000, messages from Dr. Bernstein regarding DNS cache poisoning 
attacks was also censored.  WG Chair Gudmundsson was involved in the 
censorship of those messages.


WG Chair Olafur Gudmundsson has demanded that I "agree not to engage in
personal attacks". Since I (Anderson) have never engaged in personal
attacks, this demand is based on an implied fiction. It is known as a
'loaded question' fallacy.  His demand is the same as the fallacious
question 'have you stopped beating your wife?" As in the wife-beating
fallacy, if I answer "no", then it seems as if I intend to continue
making personal attacks, implying misconduct. If I answer "yes", it
seems as if I concede to some past misconduct, also implying misconduct.  
WG Chair Gudmundsson was previously involved in the controversial
AXFR-clarify draft promoted by the BIND Cartel and was involved in the
deception of the DNSEXT WG over 1999-2002 through (at least) the
censorship of Dr. Dan Bernstein, who opposed the draft.

WG Chair Sullivan has specifically asserted that only technical messages
can be posted to DNSEXT, denying that RFC3979 compliance, financial
considerations, or discussion of the integrity of the process were
appropriate subject matter. Recently appointed, WG Chair Andrew Sullivan
has no relevant DNS experience, nor any long IETF experience. Sullivan
has been a system administrator at Affilias for a few years, and was a
protoge of Joe Abley, former ISC architech of DNS Anycast.  Sullivan had
also recently taken over the dubious IN-ADDR Required draft on DNSOP,
renamed "Considerations for the use of DNS Reverse Mapping", but
containing the same discredited claims as the IN-ADDR Required draft.

This abuse has to stop.

		--Dean




> On Mon, 11 Aug 2008, David Conrad wrote:
> > 
> > > Only SSL can protect you here.
> > 
> > As Dan Kaminsky points out: "SSL certs themselves are dependent on the  
> > DNS".
> 
> Kaminsky is wrong. SSL uses DNS to obtain an IP address to connect to a
> server, and then expects the server to produce a certificate, which the
> client verifies. Spoofing DNS does not enable the attacker to obtain the
> private key to the valid certificate.  The DNS domain information placed
> in a certificate merely allows the client to determine before
> verification if it got the certificate it asked for. However the wrong
> or fake certificate won't verify unless there is a fault in the
> Certification Authority (this happened with MS some years ago). But a
> spoofed DNS name going to a wrong server results in a failure to verify
> the certificate. So SSL is NOT "dependent on DNS".
> 
> Of course, if spoofed DNS sends the SSL connection to the wrong server,
> a DOS attack still results since one didn't get to the correct server. 
> In that sense, everything a user does is dependent on DNS. 
> 
> But it is not the case that your bank information can be stolen by this
> DNS attack, as Kaminsky seems to have told the mainstream press.
> 
> 		--Dean
> 
> 


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From owner-namedroppers@ops.ietf.org  Sun Aug 17 13:34:31 2008
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From: bert hubert <bert.hubert@netherlabs.nl>
To: namedroppers@ops.ietf.org
Cc: davidu@everydns.net
Subject: EDNS PING first draft uploaded
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Hi everybody,

In the spirit of the request at the end of the Dublin meeting, David and I
have written a draft which describes a very simple EDNS PING option.

An "EDNS PING" is an EDNS option with an opaque payload, which the remote
server appends to the RRsets in a response.

Please find further details on:
http://www.ietf.org/internet-drafts/draft-hubert-ulevitch-edns-ping-00.txt

This draft aims to standardise the very bare semantics of EDNS PING, leaving
out everything that is not strictly required to implement this EDNS option.

This basically means that how people will *use* such PINGs is entirely up to
them, but may be the subject of a followup draft.

Paul Vixie generalised what needs to be done: add enough bits of entropy to
resist spoofing, withoug specifying how such bits might be gained. 

dns-0x20, EDNS PING, fall back to TCP and repeating queries are all ways to
gain bits, and might be used to meet the requirements of such a 'minimum
entropy required' document.

Kind regards,

Bert

-- 
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From owner-namedroppers@ops.ietf.org  Mon Aug 18 06:09:43 2008
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Date: Mon, 18 Aug 2008 08:56:43 -0400
From: Scott Rose <scottr@nist.gov>
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Based on Florian's comment (seconded by Paul Vixie):

  I would like to see section 3.4 updated with language like
  this:

 "If a recursive caching name server encounters a DNAME RR which
  contradicts information already in the cache (excluding CNAME
  records), it SHOULD NOT cache the DNAME RR, but it MAY cache the
  CNAME record received along with it or synthesized from the DNAME
  record, subject the rules for CNAME caching."


Added to the draft if there are no objections (so far - none).

Scott (and Wouter)
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Subject: Re: Working Group Last Call for   draft-ietf-dnsext-dnssec-rsasha256-05
References: <20080814224325.GD60819@commandprompt.com>
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Andrew Sullivan wrote:
> Dear colleagues,
> 
> Although it is one week later than we indicated at the Dublin meeting,
> this message starts a four week working group last call for "Use of
> SHA-2 algorithms with RSA in DNSKEY and RRSIG Resource Records for
> DNSSEC".  The latest draft, and the history of the document, can be
> found at
> <http://tools.ietf.org/wg/dnsext/draft-ietf-dnsext-dnssec-rsasha256/>.
> 
> The docment is intended for the standards track, and if adopted will
> become a Proposed Standard.
> 
> Please read the document carefully.  Please send any remarks you have
> about the draft to the working group mailing list.  
> 

I have read the document and I support the draft progressing along the
standards track.

However, I agree with Paul Hoffman's comment that the reference to RFC
4641 for key sizes should be dropped.  Especially considering that DNSOP
WG has opened it up for revision.

Scott


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A New Internet-Draft is available from the on-line Internet-Drafts directories.
This draft is a work item of the DNS Extensions Working Group of the IETF.


	Title           : Measures for making DNS more resilient against forged answers
	Author(s)       : B. Hubert, R. Mook
	Filename        : draft-ietf-dnsext-forgery-resilience-07.txt
	Pages           : 25
	Date            : 2008-08-14

The current Internet climate poses serious threats to the Domain Name
System.  In the interim period before the DNS protocol can be secured
more fully, measures can already be taken to harden the DNS to make
'spoofing' a recursing nameserver many orders of magnitude harder.

Even a cryptographically secured DNS benefits from having the ability
to discard bogus responses quickly, as this potentially saves large
amounts of computation.

By describing certain behaviour that has previously not been
standardised, this document sets out how to make the DNS more
resilient against accepting incorrect responses.  This document
updates RFC 1034.

A URL for this Internet-Draft is:
http://www.ietf.org/internet-drafts/draft-ietf-dnsext-forgery-resilience-07.txt

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From owner-namedroppers@ops.ietf.org  Mon Aug 18 10:19:34 2008
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[ Note: Post was moderated. ] 

Your apology on the moderation note is accepted.

		--Dean

On Thu, 14 Aug 2008, Andrew Sullivan wrote:

> Dear colleagues,
> 
> Dean Anderson has brought an error to my attention:
> 
> On Thu, Aug 14, 2008 at 04:31:52PM -0400, Dean Anderson wrote:
> > 
> > > [ Moderators note: Post was moderated, either because it was posted by
> > >    a non-subscriber, or because it was over 20K.
> > >    With the massive amount of spam, it is easy to miss and therefore
> > >    delete relevant posts by non-subscribers.
> > >    Please fix your subscription addresses. ]
> >  
> > The moderators note is false, and deceives the Working Group. I am a
> > subscriber, and the post was not over 20K.
> 
> I wish to apologise to the members of the Working Group, and to Mr
> Anderson, for my error.  Mr Anderson, as many of you may be aware, had
> his posting privileges revoked [1].  Because of that, Mr Anderson's
> post was caught in the same trap as non-subscribers' mail.  When I
> approved it, I used an incorrect mechanism.  That mechanism added the
> "Moderator's note" text you see quoted by Mr Anderson.
> 
> The inserted text is therefore my fault, and I wish to correct the
> error.  Mr Anderson's post was not moderated because of being posted
> by a non-subscriber, or because of its size.  It was moderated
> because, while Mr Anderson is a subscriber to the mailing list, he is
> not automatically allowed to post.  I should have used a different
> mechanism to approve his post (one that would not have added only that
> text).
> 
> I regret the error.  Olafur and I are currently reviewing mailing list
> administration, but this particular mistake is entirely mine.
> 
> Best regards,
> 
> Andrew
> 
> [1] http://ops.ietf.org/lists/namedroppers/namedroppers.2008/msg00149.html
> 
> 

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From owner-namedroppers@ops.ietf.org  Tue Aug 19 13:55:37 2008
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From: "George Barwood" <george.barwood@blueyonder.co.uk>
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Subject: Some observations on dns-0x20
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I have been experimenting with the technique described ( Google for =
GbDns if interested ), and have a few observations.

(1) A simple way of dealing with case sensitivity when parsing a string =
in a DNS requests is to preserve case if and only if the section is the =
Question section.

For other sections I believe that simply reducing to lower case will not =
cause any problems, at least in a recursive context, and is the simplest =
and best solution.

(2)  When checking a response, a good model is to estimate the number of =
bits of entropy (random bits) that have been retained from the original =
request ( I will refer to this as the Confidence value ).

The port number entropy should be discounted if the program may be =
behind a NAT device, unless it is known that the device preserves port =
randomization. I think this might be mentioned somewhere in the =
standard.

If unusual responses are detected ( for example incorrect IP, Question =
not copied, Question case not preserved ), the response need not be =
entirely ignored, rather a suitable discount can be applied in the =
entropy computation.

(3) A possible implementation technique is to maintain a Confidence =
field for each cache entry.
When processing a response, the Confidence value computed in (2) can be =
added in when an exactly matching cache element ( normally with expired =
TTL ) is found.

A valid cache entry is thus one which has valid TTL and valid Confidence =
value ( say 50 bits ).

The resolver loop can iterate until either a valid cache entry is found, =
or an iteration occurs in which the cache is not updated ( this includes =
updates to TTL or Confidence values ).

Non-existence and error conditions can also be cached, with confidence =
values.

Lastly, I would like to say that I strongly support dns-0x20, and have =
communicated a couple of suggested changes privately to Paul, which he =
has graciously agreed to make, viz.

(a) In section 7.4, to drop the words "by a factor of "several".
(b) In section 5.2 to change "MUST" to "SHOULD".

George Barwood
------=_NextPart_000_01BF_01C90244.4F5964A0
Content-Type: text/html;
	charset="iso-8859-1"
Content-Transfer-Encoding: quoted-printable

<!DOCTYPE HTML PUBLIC "-//W3C//DTD HTML 4.0 Transitional//EN">
<HTML><HEAD>
<META http-equiv=3DContent-Type content=3D"text/html; =
charset=3Diso-8859-1">
<META content=3D"MSHTML 6.00.6000.16705" name=3DGENERATOR>
<STYLE></STYLE>
</HEAD>
<BODY bgColor=3D#ffffff>
<DIV><FONT face=3DArial size=3D2>
<DIV><FONT face=3DArial size=3D2>I have been experimenting with the =
technique=20
described ( Google for GbDns if interested ), and have a few=20
observations.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>(1) A simple way of dealing with case =
sensitivity=20
when parsing a string in a DNS requests is to preserve case if and only =
if the=20
section is the Question section.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>For other sections I believe that =
simply reducing=20
to lower case will not cause any problems, at least in a recursive =
context, and=20
is the simplest and best solution.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>(2)&nbsp; When checking a response, a =
good model is=20
to estimate the number of bits of entropy (random bits) that have been =
retained=20
from the original request ( I will refer to this as the Confidence value =

).</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>The port number entropy should be =
discounted if=20
the&nbsp;program&nbsp;may be behind a NAT device, unless it is known =
that the=20
device preserves port randomization. I think this&nbsp;might be =
mentioned=20
somewhere in the standard.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>If unusual responses are detected ( for =
example=20
incorrect IP, Question not copied, Question case not preserved ), the =
response=20
need not be entirely ignored, rather a suitable discount can be applied =
in the=20
entropy computation.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>(3)&nbsp;A&nbsp;possible implementation =
technique=20
is to maintain a Confidence field for each cache entry.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2>When processing a response, the =
Confidence value=20
computed in (2) can be added in when an exactly matching cache element ( =

normally with expired TTL ) is found.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>A valid cache entry is thus one which =
has valid TTL=20
and valid Confidence value ( say 50 bits ).</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>The resolver loop can iterate until =
either a valid=20
cache entry is found, or&nbsp;an iteration occurs in which the cache is =
not=20
updated ( this includes updates to TTL or Confidence values =
).</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>Non-existence and error conditions can =
also be=20
cached, with confidence values.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>Lastly, I would like to say that I =
strongly support=20
dns-0x20, and have communicated a couple of&nbsp;suggested changes =
privately to=20
Paul, which he has graciously agreed to make, viz.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>(a) In section 7.4, to drop the words =
"by a factor=20
of "several".</FONT></DIV>
<DIV><FONT face=3DArial size=3D2>(b) In section 5.2 to change "MUST" to=20
"SHOULD".</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>George=20
Barwood</FONT></DIV></FONT></DIV></BODY></HTML>

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Subject: Re: deprecating dangerous bit patterns and non-TC non-AXFR
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i started a thread on dnsop that really belongs on namedroppers.  moving it.

florian weimer wrote, quoting paul vixie:

> [QTYPE=ANY deprecation]
> 
> > so, can you explain what you mean by "breaks", both for sendmail and
> > qmail?
> 
> I thought deprecation means that responders (especially resolvers) are
> free to discard such queries.  At least that's how the binary label
> deprecation was interpreted by some folks.  I don't see how this would
> be different, at least for resolvers.

i propose that an empty answer be sent, so that anyone waiting on it
would know to move on to their next state.

> [QCLASS != IN deprecation]
> 
> > i don't think we should foreclose the possibility that QCLASS != IN
> > will be useful to somebody some day.  do you know a specific risk
> > for QCLASS != IN?
> 
> Reducing the arbitrariness of the DNS header reduces the risk that you
> run into a query/response loop with some other service (like chargen
> or time).

that's not a specific enough risk to warrant outlawing a bit pattern, imho.

> >> > 	RA=1 AND RD=0
> >> 
> >> By the responder or the initiator?
> >
> > nonrecursive queries of recursive servers [snip]
> 
> Ahem, my concern was that the RA bit is set by the responder, while
> the RD bit is set by the initiator.  RA=1 *queries* don't make much
> sense, no matter what the RD bit is.  As Peter Koch noted, RA=1, RD=0
> responses occur in the wild.  So I was confused.

so you're OK with my proposal that if a responder has no authority data
matching the question and RD=0 that it should send back an empty answer?

> [DNS over TCP deprecation]
> 
> >> I strongly oppose this approach.  Unsolicited TCP has its place.
> >
> > are you strongly in favour of amending RFC 1035 4.2.2 to say that
> > responders initiate close, or that timeouts of less than two minutes
> > are allowed?
> 
> No need to update RFC 1035, RFC 1123 already did that: "A name server
> MAY limit the resources it devotes to TCP queries" (section 6.1.3.2).

its justification for this is the 512 octet barrier then in force, and so
i can see that this text should have been explicitly modified by RFC 2671
since there is now a well defined non-TCP method of crossing that barrier.

however, that section also begins as follows:

         6.1.3.2  Transport Protocols

            DNS resolvers and recursive servers MUST support UDP, and
            SHOULD support TCP, for sending (non-zone-transfer) queries.

so, TCP/53 is already optional, which explains why so many people treat
it as optional.  word on the street is, if you're not answering AXFR and
you never set the TC bit in UDP/53, you don't have to implement TCP/53.
what i didn't realize until you referenced RFC 1123 6.1.3.2, is that this
isn't just the word on the street, it's well supported in the scriptures.

anyone who proposes TCP/53 as a fallback during keyhole attacks, take note:
it's not required; and if implemented, it's incredibly vulnerable to attack;
and in any case it will not scale.

> > did RDP (RFC 908, RFC 1151) ever achieve critical mass?
> 
> Not likely, given that the acronym has been reused for something totally
> different.  I think for reliable datagram transport with some deployment,
> you need to use SCTP.  I've never seen this RDP in the wild.

ok, same question then.  is SCTP something we should consider as a way out
of our bad choice between IP fragmentation and TCP for messages larger than
the MTU?  <http://en.wikipedia.org/wiki/Stream_Control_Transmission_Protocol>
makes it sound safe and wonderful.  "man 4 sctp" on FreeBSD looks healthy.

as always, my big concern is "what will the middleboxes do?"

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From owner-namedroppers@ops.ietf.org  Wed Aug 20 09:59:38 2008
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Subject: Re: deprecating dangerous bit patterns and non-TC non-AXFR
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From: Florian Weimer <fweimer@bfk.de>
Date: Wed, 20 Aug 2008 18:54:20 +0200
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* Paul Vixie:

> i propose that an empty answer be sent

What can stand as an empty answer?  REFUSED?

As a general rule, I think we shouldn't generate new cases where we
don't echo back the question section.

> so you're OK with my proposal that if a responder has no authority
> data matching the question and RD=3D0 that it should send back an
> empty answer?

I think this was previously discussed on namedroppers, and there
wasn't any consensus back then.  (Another option besides REFUSED is
referral to the root.)

[DNS over TCP]

>          6.1.3.2  Transport Protocols
>
>             DNS resolvers and recursive servers MUST support UDP, and
>             SHOULD support TCP, for sending (non-zone-transfer) queries.
>
> so, TCP/53 is already optional, which explains why so many people treat
> it as optional.=20

According to the quoted sentence, is optional on the initiator, not on
the responder.  However, operators treat it as if it were optional on
the responder.

> word on the street is, if you're not answering AXFR and you never
> set the TC bit in UDP/53, you don't have to implement TCP/53.

Yes, but I think this is wrong.  Read on:

  A name server [...] SHOULD NOT refuse to service a TCP query just
  because it would have succeeded with UDP.

Generally filtering TCP queries is against that recommendation.

> what i didn't realize until you referenced RFC 1123 6.1.3.2, is that
> this isn't just the word on the street, it's well supported in the
> scriptures.

I've been beating this drum for years, but there's this bizarre
assumption that RFC 1123 is not as normative as RFC 1035. 8-/

> is SCTP something we should consider as a way out

No, it's not.

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=DFe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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From owner-namedroppers@ops.ietf.org  Wed Aug 20 10:34:52 2008
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Date: Wed, 20 Aug 2008 19:28:00 +0200
From: Mohsen Souissi <mohsen.souissi@nic.fr>
To: Paul Vixie <vixie@isc.org>
Cc: namedroppers@ops.ietf.org
Subject: Re: deprecating dangerous bit patterns and non-TC non-AXFR
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Paul,

Please let me comment on the way your note below:

 On 20 Aug, Paul Vixie wrote:
[...]

 | 
 | > [DNS over TCP deprecation]
 | > 
 | > >> I strongly oppose this approach.  Unsolicited TCP has its place.
 | > >
 | > > are you strongly in favour of amending RFC 1035 4.2.2 to say that
 | > > responders initiate close, or that timeouts of less than two minutes
 | > > are allowed?
 | > 
 | > No need to update RFC 1035, RFC 1123 already did that: "A name server
 | > MAY limit the resources it devotes to TCP queries" (section 6.1.3.2).
 | 
 | its justification for this is the 512 octet barrier then in force, and so
 | i can see that this text should have been explicitly modified by RFC 2671
 | since there is now a well defined non-TCP method of crossing that barrier.
 | 
 | however, that section also begins as follows:
 | 
 |          6.1.3.2  Transport Protocols
 | 
 |             DNS resolvers and recursive servers MUST support UDP, and
 |             SHOULD support TCP, for sending (non-zone-transfer) queries.
 | 
 | so, TCP/53 is already optional, which explains why so many people treat
 | it as optional.  word on the street is, if you're not answering AXFR and
 | you never set the TC bit in UDP/53, you don't have to implement TCP/53.
 | what i didn't realize until you referenced RFC 1123 6.1.3.2, is that this
 | isn't just the word on the street, it's well supported in the scriptures.
 | 
 | anyone who proposes TCP/53 as a fallback during keyhole attacks, take note:
                                                                    ^^^^^^^^^
 | it's not required; and if implemented, it's incredibly vulnerable to attack;
   ^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^
 | and in any case it will not scale.
   ^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^^

I agree with you that supporting EDNS0 (RFC 2671) is far much better
and scalable than TCP fallback in case od DNS response size exceeding
512 octets.

Note that same section 6.1.3.2 says:

"However, it is also clear that some new DNS record types defined in
the future will contain information exceeding the 512 byte limit that
applies to UDP, and hence will require TCP.  Thus, resolvers and name
                               ^^^^^^^^^^^
servers should implement TCP services as a backup to UDP today, with
the knowledge that they will require the TCP service in the future."
                             ^^^^^^^

As RFC 2671 could have made EDNS0 a MUST and TCP fallback simply
deprecated when EDNS0 has taken over (but it actually didn't), I think
we have reached today that "future" with IPv6 and DNSSEC each alone
or combined (worse!).

So unless, all intermediate entities from the stub-resolver to the
ADNS are EDNS0-capable, TCP fallback stays the only possible solution
to get a valid (complete) DNS response back to the stub-resolver *if*
the response size exceeds 512 octets.

Shouldn't your warning above at least equally stress the importance of
EDNS0 being deployed throughout the DNS resolution chain (including
middle-systems like NATs/firewall et al.)?

Hence, does this re-wording proposal make sense?

"You MUST support EDNS0 on all your DNS components. 

- If/when you have done it, then you MAY (SHOULD?) stop supporting TCP
  for non XFR activity (still MUST for XFR),

- If you don't support it (for whatever reason), then you SHOULD
  (MUST?) support TCP as a fallback facility for resolution activity
  (still MUST for XFR)."



So why am I bringing this?

1) I'm simply afraid that some ISPs or other vendors who will read you
and who will not support EDNS0 (for whatever reason), will also
(continue to) block TCP fallback, thus denying DNS service to their
customers should the response size exceed 512 octets.

2) It is directly related to the discussion which took place on dnsext ml
while editing dns-protocol-profile:
http://www.ops.ietf.org/lists/namedroppers/namedroppers.2008/msg00037.html
(see section 4.2.2).

The I-D expired on Jul 22nd, a copy is available here:
http://ietfreport.isoc.org/idref/draft-ietf-dnsext-dns-protocol-profile/

This I-D should be recycled in the near future as I understood from
last dnsext session @ IETF. And then, the result of the current debate
may be helpful for people in charge of editing next version dns-protocol-profile...


Mohsen.


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From owner-namedroppers@ops.ietf.org  Wed Aug 20 11:30:36 2008
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> > i propose that an empty answer be sent
> 
> What can stand as an empty answer?  REFUSED?

ANCOUNT=0

> As a general rule, I think we shouldn't generate new cases where we
> don't echo back the question section.

the question section MUST be present or the answer won't be recognized.

> >          6.1.3.2  Transport Protocols
> >
> >             DNS resolvers and recursive servers MUST support UDP, and
> >             SHOULD support TCP, for sending (non-zone-transfer) queries.
> >
> > so, TCP/53 is already optional, which explains why so many people treat
> > it as optional. 
> 
> According to the quoted sentence, is optional on the initiator, not on
> the responder.  However, operators treat it as if it were optional on
> the responder.

it says "and servers" and means it.  there's a restatement later on:

            DNS servers MUST be able to service UDP queries and SHOULD
            be able to service TCP queries.

i think the authors showed in this sentence that they knew the difference
between SHOULD and MUST, and chose with their eyes wide open.  not that we
have to grant these authors omniscience, but these are the unambiguous words
that have guided the installed base.

> > word on the street is, if you're not answering AXFR and you never
> > set the TC bit in UDP/53, you don't have to implement TCP/53.
> 
> Yes, but I think this is wrong.  Read on:
> 
>   A name server [...] SHOULD NOT refuse to service a TCP query just
>   because it would have succeeded with UDP.
> 
> Generally filtering TCP queries is against that recommendation.

while it strongly implies that one's intention to never truncate is not
grounds in and of itself to not implement TCP, it still says SHOULD not
MUST, leaving it up to the implementors or operators of responders (or
their firewalls) to leave out TCP and still be completely compliant with
RFC 1123.

> > is SCTP something we should consider as a way out
> 
> No, it's not.

can you say more?


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To: Paul Vixie <vixie@isc.org>, Florian Weimer <fweimer@bfk.de>
From: Olafur Gudmundsson <ogud@ogud.com>
Subject: Re: deprecating dangerous bit patterns and non-TC non-AXFR
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<no-hat>
At 14:24 20/08/2008, Paul Vixie wrote:
> > > i propose that an empty answer be sent
> >
> > What can stand as an empty answer?  REFUSED?
>
>ANCOUNT=0

RCODE=REFUSED seems to me to be a cleaner solution and as nameserver
are allowed to send that back any time it likes, this is not even a
hit of protocol change.
Someone can just write a short document
"QTYPE=ANY considered harmful, just REFUSE them"  :-)
to document the practice and point the people at that complain.


Root referral is UGLY and misleading.
> > > is SCTP something we should consider as a way out
> >
> > No, it's not.
>
>can you say more?

After looking at using SCTP for DNS,
I kind of agree with Florian but it would be nice if someone that understands
the details of the different transport protocols would tell us why.

         Olafur


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> Shouldn't your warning above at least equally stress the importance of
> EDNS0 being deployed throughout the DNS resolution chain (including
> middle-systems like NATs/firewall et al.)?

Many SOHO NATs are somewhat broken with respect to EDNS0, at least 
whenever their built-in ALGs are used (as is normally the case according 
to default DHCP settings).

I'm going to be offline for the next week, but very shortly thereafter the 
report on DNSSEC compatibility in SOHO CPE that I and another researcher 
have been working on will be published with all the gory details.  I'll 
also be presenting this at the OARC Workshop on September 24th.

Another consideration is that both Bind and Unbound cap their UDP TX 
packet size to 4096 bytes, regardless of how high the client's OPT RR 
receive packet size is.  That, at least, is easily fixed.

Ray

-- 
Ray Bellis, MA(Oxon)
Senior Researcher in Advanced Projects, Nominet
e: ray@nominet.org.uk, t: +44 1865 332211


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From owner-namedroppers@ops.ietf.org  Wed Aug 20 16:50:49 2008
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To: Paul Vixie <vixie@isc.org>
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: deprecating dangerous bit patterns and non-TC non-AXFR 
In-reply-to: Your message of "Wed, 20 Aug 2008 18:24:15 GMT."
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> > > i propose that an empty answer be sent
> > 
> > What can stand as an empty answer?  REFUSED?
> 
> ANCOUNT=0
> 
> > As a general rule, I think we shouldn't generate new cases where we
> > don't echo back the question section.
> 
> the question section MUST be present or the answer won't be recognized.
> 
> > >          6.1.3.2  Transport Protocols
> > >
> > >             DNS resolvers and recursive servers MUST support UDP, and
> > >             SHOULD support TCP, for sending (non-zone-transfer) queries.
> > >
> > > so, TCP/53 is already optional, which explains why so many people treat
> > > it as optional. 
> > 
> > According to the quoted sentence, is optional on the initiator, not on
> > the responder.  However, operators treat it as if it were optional on
> > the responder.
> 
> it says "and servers" and means it.  there's a restatement later on:
> 
>             DNS servers MUST be able to service UDP queries and SHOULD
>             be able to service TCP queries.
> 
> i think the authors showed in this sentence that they knew the difference
> between SHOULD and MUST, and chose with their eyes wide open.  not that we
> have to grant these authors omniscience, but these are the unambiguous words
> that have guided the installed base.
> 
> > > word on the street is, if you're not answering AXFR and you never
> > > set the TC bit in UDP/53, you don't have to implement TCP/53.
> > 
> > Yes, but I think this is wrong.  Read on:
> > 
> >   A name server [...] SHOULD NOT refuse to service a TCP query just
> >   because it would have succeeded with UDP.
> > 
> > Generally filtering TCP queries is against that recommendation.
> 
> while it strongly implies that one's intention to never truncate is not
> grounds in and of itself to not implement TCP, it still says SHOULD not
> MUST, leaving it up to the implementors or operators of responders (or
> their firewalls) to leave out TCP and still be completely compliant with
> RFC 1123.

I seriously doubt that most firewall admins that turn off DNS/TCP
have put the requisite thought into the process to meet the
requirements levels to break a SHOULD.

The number of times that it is justified by "TCP is only used for
AXFR" make it clear that the care and thought that should have been
applied wasn't.
 
> > > is SCTP something we should consider as a way out
> > 
> > No, it's not.
> 
> can you say more?
> 
> 
> -- 
> This message has been scanned for viruses and
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> 
> 
> --
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1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Wed Aug 20 17:27:35 2008
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        namedroppers@ops.ietf.org
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: deprecating dangerous bit patterns and non-TC non-AXFR 
In-reply-to: Your message of "Wed, 20 Aug 2008 16:05:11 -0400."
             <200808202005.m7KK5V9Q074537@stora.ogud.com> 
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> 
> 
> <no-hat>
> At 14:24 20/08/2008, Paul Vixie wrote:
> > > > i propose that an empty answer be sent
> > >
> > > What can stand as an empty answer?  REFUSED?
> >
> >ANCOUNT=0
> 
> RCODE=REFUSED seems to me to be a cleaner solution and as nameserver
> are allowed to send that back any time it likes, this is not even a
> hit of protocol change.
> Someone can just write a short document
> "QTYPE=ANY considered harmful, just REFUSE them"  :-)
> to document the practice and point the people at that complain.

	We have load balancers that send REFUSED rather than NOERROR
	for AAAA queries today.  These cause operational problems.
 
> Root referral is UGLY and misleading.
> > > > is SCTP something we should consider as a way out
> > >
> > > No, it's not.
> >
> >can you say more?
> 
> After looking at using SCTP for DNS,
> I kind of agree with Florian but it would be nice if someone that understands
> the details of the different transport protocols would tell us why.
> 
>          Olafur
> 
> 
> --
> to unsubscribe send a message to namedroppers-request@ops.ietf.org with
> the word 'unsubscribe' in a single line as the message text body.
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1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Wed Aug 20 20:44:18 2008
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RFC 1034 states:

    Each secondary server is required to perform the following operations
    against the master, but may also optionally perform these operations
    against other secondary servers.  This strategy can improve the transfer
    process when the primary is unavailable due to host downtime or network
    problems, or when a secondary server has better network access to an
    "intermediate" secondary than to the primary.

      

Now, disregarding the obsolete "secondary" language (we now call them 
"slaves"), and the obviously-incorrect word "following" (which can't 
possibly be right, since this is the last paragraph of the section -- 
there is nothing relevant "following"), one notes the blatant ambiguity 
of "these operations". Which operations? Minimally, checking the serial 
number and performing a zone transfer if it has increased? I think that 
much is fairly obvious.

What's a little *less* obvious, and the point of my missive, is whether, 
when and/or how "these operations" might include the following, from a 
previous paragraph: "

If the secondary finds it impossible to perform a serial check for the EXPIRE interval, it must 
assume that its copy of the zone is obsolete an[sic] discard it."

The problem with slaves resetting their EXPIRE timers every time they 
perform a successful refresh from another slave is that the slaves may 
be in a reciprocal or circular -- A refreshes from B, B refreshes from 
C, C refreshes from A -- relationship, so the zone may become 
"immortal", i.e. even when it is deleted from the primary master, the 
slaves continue to keep the zone alive indefinitely by constantly 
refreshing each other.

Surely it cannot have been the intent for zones to become "immortal". 
That would defeat the whole purpose of having EXPIRE in the first place.

Yet, having slaves in a reciprocal or circular relationship is a 
perfectly _valid_ arrangement. It ensures that, if the primary master 
goes down for an extended period of time (i.e. multiple REFRESH cycles), 
all slaves in the set eventually converge on the latest-available 
version of the zone.

I would suggest, therefore, that if this language in 1034 cannot or will 
not be clarified/updated in the foreseeable future, so as to outlaw this 
"optional" replication topology, that implementors review their 
refresh/expire logic, and if it doesn't already exist in their 
implementation, provide a way for administrators to differentiate true 
"master" replication sources, which reset the EXPIRE timer on each 
successful refresh, from "peer"  sources, which do not. This would allow 
large enterprises --such as ours -- to build highly robust and available 
DNS infrastructures without having to struggle with zone-immortality 
risks/issues.

                                                                         
                  - Kevin



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From owner-namedroppers@ops.ietf.org  Wed Aug 20 21:35:01 2008
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To: Kevin Darcy <kcd@chrysler.com>
Cc: namedroppers@ops.ietf.org
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: Zone Immortality 
In-reply-to: Your message of "Wed, 20 Aug 2008 23:32:38 -0400."
             <48ACE1D6.20708@chrysler.com> 
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> RFC 1034 states:
> 
>     Each secondary server is required to perform the following operations
>     against the master, but may also optionally perform these operations
>     against other secondary servers.  This strategy can improve the transfer
>     process when the primary is unavailable due to host downtime or network
>     problems, or when a secondary server has better network access to an
>     "intermediate" secondary than to the primary.
> 
>       
> 
> Now, disregarding the obsolete "secondary" language (we now call them 
> "slaves"), and the obviously-incorrect word "following" (which can't 
> possibly be right, since this is the last paragraph of the section -- 
> there is nothing relevant "following"), one notes the blatant ambiguity 
> of "these operations". Which operations? Minimally, checking the serial 
> number and performing a zone transfer if it has increased? I think that 
> much is fairly obvious.
> 
> What's a little *less* obvious, and the point of my missive, is whether, 
> when and/or how "these operations" might include the following, from a 
> previous paragraph: "
> 
> If the secondary finds it impossible to perform a serial check for the EXPIRE
>  interval, it must 
> assume that its copy of the zone is obsolete an[sic] discard it."
> 
> The problem with slaves resetting their EXPIRE timers every time they 
> perform a successful refresh from another slave is that the slaves may 
> be in a reciprocal or circular -- A refreshes from B, B refreshes from 
> C, C refreshes from A -- relationship, so the zone may become 
> "immortal", i.e. even when it is deleted from the primary master, the 
> slaves continue to keep the zone alive indefinitely by constantly 
> refreshing each other.
> 
> Surely it cannot have been the intent for zones to become "immortal". 
> That would defeat the whole purpose of having EXPIRE in the first place.
> 
> Yet, having slaves in a reciprocal or circular relationship is a 
> perfectly _valid_ arrangement. It ensures that, if the primary master 
> goes down for an extended period of time (i.e. multiple REFRESH cycles), 
> all slaves in the set eventually converge on the latest-available 
> version of the zone.
> 
> I would suggest, therefore, that if this language in 1034 cannot or will 
> not be clarified/updated in the foreseeable future, so as to outlaw this 
> "optional" replication topology, that implementors review their 
> refresh/expire logic, and if it doesn't already exist in their 
> implementation, provide a way for administrators to differentiate true 
> "master" replication sources, which reset the EXPIRE timer on each 
> successful refresh, from "peer"  sources, which do not. This would allow 
> large enterprises --such as ours -- to build highly robust and available 
> DNS infrastructures without having to struggle with zone-immortality 
> risks/issues.
> 
>                                                                          
>                   - Kevin

	There are lots of existing ways to address this.

	* Outlaw loops.
	* Don't reset the expire counter on refresh from peers only
	  on transfer from peers.

	* Use DNSSEC to make data go stale.

	Extend AXFR/IXFR/SOA to add a expiry counter.  The master would
	always set this to SOA EXPIRE.  The slave would report it's
	current value for that counter.

	This fits well into EDNS as it is a hop-by-hop value.

	It would also address the N * expiry problem that currently
	exists when you have a deep transfer graph.

	e.g.  <EXPIRE><4><COUNTER>

	The slave would add a <EXPIRE><0> option to its SOA
	refresh queries and to IXFR and AXFR queries.

	The slave would use the maximum of the returned value and
	it's expire counter on SOA serial matches to refresh queries
	or IXFR up to date responses to set its expire counter.

	The slave would use this value rather than the SOA expire
	field to initialise it's expire counter on IXFR/AXFR which
	change the zone content.

	The slave will perform a sanity check to ensure that the
	returned value is no greater than the SOA expire field.  If
	it is greater then it will use the SOA expire field instead.

	Mark
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Wed Aug 20 22:11:02 2008
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To: Kevin Darcy <kcd@chrysler.com>
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Kevin Darcy wrote:
> RFC 1034 states:
>
>    Each secondary server is required to perform the following operations
>    against the master, but may also optionally perform these operations
>    against other secondary servers.  This strategy can improve the 
> transfer
>    process when the primary is unavailable due to host downtime or 
> network
>    problems, or when a secondary server has better network access to an
>    "intermediate" secondary than to the primary.
>
>     
> Now, disregarding the obsolete "secondary" language (we now call them 
> "slaves"), and the obviously-incorrect word "following" (which can't 
> possibly be right, since this is the last paragraph of the section -- 
> there is nothing relevant "following"), one notes the blatant 
> ambiguity of "these operations". Which operations? Minimally, checking 
> the serial number and performing a zone transfer if it has increased? 
> I think that much is fairly obvious.
>
> What's a little *less* obvious, and the point of my missive, is 
> whether, when and/or how "these operations" might include the 
> following, from a previous paragraph: "
>
> If the secondary finds it impossible to perform a serial check for the 
> EXPIRE interval, it must assume that its copy of the zone is obsolete 
> an[sic] discard it."
>
> The problem with slaves resetting their EXPIRE timers every time they 
> perform a successful refresh from another slave is that the slaves may 
> be in a reciprocal or circular -- A refreshes from B, B refreshes from 
> C, C refreshes from A -- relationship, so the zone may become 
> "immortal", i.e. even when it is deleted from the primary master, the 
> slaves continue to keep the zone alive indefinitely by constantly 
> refreshing each other.
>
> Surely it cannot have been the intent for zones to become "immortal". 
> That would defeat the whole purpose of having EXPIRE in the first place.
>
> Yet, having slaves in a reciprocal or circular relationship is a 
> perfectly _valid_ arrangement. It ensures that, if the primary master 
> goes down for an extended period of time (i.e. multiple REFRESH 
> cycles), all slaves in the set eventually converge on the 
> latest-available version of the zone.
>
> I would suggest, therefore, that if this language in 1034 cannot or 
> will not be clarified/updated in the foreseeable future, so as to 
> outlaw this "optional" replication topology, that implementors review 
> their refresh/expire logic, and if it doesn't already exist in their 
> implementation, provide a way for administrators to differentiate true 
> "master" replication sources, which reset the EXPIRE timer on each 
> successful refresh, from "peer"  sources, which do not. This would 
> allow large enterprises --such as ours -- to build highly robust and 
> available DNS infrastructures without having to struggle with 
> zone-immortality risks/issues.

It raises an interesting question, if more than one slave transfers the 
zone with the same serial. Should all subsequent transfers from those 
slaves necessarily get the same result (i.e. related to EXPIRE timer 
logic), or perhaps whichever of the slaves transfered the zone *last*, 
would legitimately have a slightly better value (since its own EXPIRE 
timer started ticking later)?

Here's my suggestion:

If a zone is transfered *from* a slave, the values for the TTLs should 
be modified downwards by the local EXPIRE timer. Only transfers from a 
zone master should have the original TTL values from the SOA used for 
timers.

This would mean that all recipients of a transfer from a slave would 
have EXPIRE timers that fire at the same time as the slave - effectively 
synchronizing the expiry for any slave^n-th that doesn't succeed in 
doing a refresh from some source with a better SOA SN *or* EXPIRE timer.

It basically functions analogously to NTP source "stratum", where 
stratum is monotonically increasing across peerings...

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From owner-namedroppers@ops.ietf.org  Wed Aug 20 22:57:46 2008
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To: Kevin Darcy <kcd@chrysler.com>
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Kevin Darcy wrote:

> all slaves in the set eventually converge on the latest-available 
> version of the zone.

A hidden assumption of 1034 is that such convergence will occur
within a period much shorter than the expiration period.

If not, you have an administrative problem a lot more serious
than a small variation of expiraiton period.

							Masataka Ohta


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Subject: Some observations on dns-0x20
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[ Moderators note: Post was moderated, either because it was posted by
   a non-subscriber, or because it was over 20K.  
   With the massive amount of spam, it is easy to miss and therefore 
   delete relevant posts by non-subscribers. 
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I have been experimenting with the technique described ( Google for GbDns i=
f interested ), and have a few observations.

(1) A simple way of dealing with case sensitivity when parsing a string in =
a DNS requests is to preserve case if and only if the section is the Questi=
on section.

For other sections I believe that simply reducing to lower case will not ca=
use any problems, at least in a recursive context, and is the simplest and =
best solution.

(2)  When checking a response, a good model is to estimate the number of bi=
ts of entropy (random bits) that have been retained from the original reque=
st ( I will refer to this as the Confidence value ).

The port number entropy should be discounted if the program may be behind a=
 NAT device, unless it is known that the device preserves port randomizatio=
n. I think this might be mentioned somewhere in the standard.

If unusual responses are detected ( for example incorrect IP, Question not =
copied, Question case not preserved ), the response need not be entirely ig=
nored, rather a suitable discount can be applied in the entropy computation.

(3) A possible implementation technique is to maintain a Confidence field f=
or each cache entry.
When processing a response, the Confidence value computed in (2) can be add=
ed in when an exactly matching cache element ( normally with expired TTL ) =
is found.

A valid cache entry is thus one which has valid TTL and valid Confidence va=
lue ( say 50 bits ).

The resolver loop can iterate until either a cache entry is found, or an it=
eration occurs in which the cache is not updated ( this includes updates to=
 TTL or Confidence values ).

Non-existence and error conditions can also be cached, with confidence valu=
es.

Lastly, I would like to say that I strongly support dns-0x20, and have comm=
unicated a couple of suggested changes privately to Paul, which he has grac=
iously agreed to make, viz.

(a) In section 7.4, to drop the words "by a factor of "several".
(b) In section 5.2 to change "MUST" to "SHOULD".

George Barwood

=20

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<STYLE></STYLE>
</HEAD>
<BODY bgColor=3D#ffffff>
<DIV><FONT face=3DArial size=3D2>I have been experimenting with the techniq=
ue=20
described ( Google for GbDns if interested ), and have a few=20
observations.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>(1) A simple way of dealing with case sens=
itivity=20
when parsing a string in a DNS requests is to preserve case if and only if =
the=20
section is the Question section.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>For other sections I believe that simply r=
educing=20
to lower case will not cause any problems, at least in a recursive context,=
 and=20
is the simplest and best solution.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>(2)&nbsp; When checking a response, a good=
 model is=20
to estimate the number of bits of entropy (random bits) that have been reta=
ined=20
from the original request ( I will refer to this as the Confidence value=20
).</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>The port number entropy should be discount=
ed if=20
the&nbsp;program&nbsp;may be behind a NAT device, unless it is known that t=
he=20
device preserves port randomization. I think this&nbsp;might be mentioned=
=20
somewhere in the standard.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>If unusual responses are detected ( for ex=
ample=20
incorrect IP, Question not copied, Question case not preserved ), the respo=
nse=20
need not be entirely ignored, rather a suitable discount can be applied in =
the=20
entropy computation.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>(3)&nbsp;A&nbsp;possible implementation te=
chnique=20
is to maintain a Confidence field for each cache entry.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2>When processing a response, the Confidence=
 value=20
computed in (2) can be added in when an exactly matching cache element (=20
normally with expired TTL ) is found.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>A valid cache entry is thus one which has =
valid TTL=20
and valid Confidence value ( say 50 bits ).</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>The resolver loop can iterate until either=
 a cache=20
entry is found, or&nbsp;an iteration occurs in which the cache is not updat=
ed (=20
this includes updates to TTL or Confidence values ).</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>Non-existence and error conditions can als=
o be=20
cached, with confidence values.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>Lastly, I would like to say that I strongl=
y support=20
dns-0x20, and have communicated a couple of&nbsp;suggested changes privatel=
y to=20
Paul, which he has graciously agreed to make, viz.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>(a) In section 7.4, to drop the words "by =
a factor=20
of "several".</FONT></DIV>
<DIV><FONT face=3DArial size=3D2>(b) In section 5.2 to change "MUST" to=20
"SHOULD".</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>George Barwood</FONT></DIV><br><br>
<P align=3Dcenter>&nbsp;&nbsp;</P>
</body></HTML>

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From: Francis Dupont <Francis.Dupont@fdupont.fr>
To: Olafur Gudmundsson <ogud@ogud.com>
cc: Paul Vixie <vixie@isc.org>, Florian Weimer <fweimer@bfk.de>,
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Subject: Re: deprecating dangerous bit patterns and non-TC non-AXFR 
In-reply-to: Your message of Wed, 20 Aug 2008 16:05:11 EDT.
             <200808202005.m7KK5V9Q074537@stora.ogud.com> 
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 In your previous mail you wrote:

   >can you say more?
   
   After looking at using SCTP for DNS,

   I kind of agree with Florian but it would be nice if someone that
   understands the details of the different transport protocols would
   tell us why.
   
=> IMHO DCCP is a better candidate but what we need is a transaction
oriented transport... As far as I know the last proposal was T/TCP
and nothing serious emerged after even there is a "market" for this.

A workshop at the next IETF?

Regards

Francis.Dupont@fdupont.fr

PS: for SCTP none of the nice features of SCTP has an interest for the
common DNS (i.e., the part which uses UDP when the payload is not over
sized, not AXFR where SCTP makes sense). As these features are not
always for free SCTP has no definitive advantage over TCP and clearly
can't take the place of UDP (for DNS).

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--=-=-=

Francis Dupont <Francis.Dupont@fdupont.fr>:

> Olafur Gudmundsson <ogud@ogud.com>:
> 
>    I kind of agree with Florian but it would be nice if someone that
>    understands the details of the different transport protocols would
>    tell us why.
>    
> => IMHO DCCP is a better candidate but what we need is a transaction
> oriented transport... As far as I know the last proposal was T/TCP
> and nothing serious emerged after even there is a "market" for this.

here are two articles on dnsop by bill fumerola in response to this thread
there.  since sctp is slightly older and is used in ip telephony and is
implemented on more systems and allows data transfer on the second round
trip (packets 3 and 4), i'm more hopeful for it than i am for DCCP.

> A workshop at the next IETF?

i'd like to make significant progress by e-mail, open workshops, and
concalls, rather than gating progress to thrice-yearly IETF meetings.  i
know i said that in the MODA proceedings, but i've since then been proved
right, but now we've seen a 10-hour attack against the only mitigation
we've got.  we won't have MODA but we can gather interested parties and get
significant work done in between IETF meetings now that we're all motivated.

> PS: for SCTP none of the nice features of SCTP has an interest for the
> common DNS (i.e., the part which uses UDP when the payload is not over
> sized, not AXFR where SCTP makes sense). As these features are not
> always for free SCTP has no definitive advantage over TCP and clearly
> can't take the place of UDP (for DNS).

i see five reasons why SCTP is worth looking at as a primary transport with
UDP as its fallback.  first, data transfer can take place in the second
round trip (packets 3 and 4).  second, it has 32-bit ID fields so we could
go back to fixed port numbers perhaps even fixed+increment on TXID's.
third, we could mandate EDNS, and with it, we could mandate PING.  fourth,
SCTP has the idea of "passive" sockets which mean nonquadratic socket pool
sizes.  fifth, association timeout is handled in the stack not the app.

i see two gigantic challenges for ANY non-UDP transport: installed base of
DNS protocol agents; installed base of firewalls and NATs and middleboxes.

here's bill fumerola's text from dnsop.  two messages attached:


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On Wed, Aug 20, 2008 at 02:41:41PM +0000, Paul Vixie wrote:
> with rich stevens gone and nobody to complete or champion T/TCP, we're left
> with several bad multipacket protocols including IP fragmentation and TCP for
> handling data larger than the MTU.  i don't know how to make TCP scale for
> this, it's not like TCP/80 where server operators who want to handle a million
> simultaneous queries know that they'll need a lot of silicon+power to do it.

http://tools.ietf.org/html/draft-agl-tcpm-sadata-01
https://datatracker.ietf.org/drafts/draft-agl-tcpm-sadata/

i'm not advocating for or against this I-D or willing to predict its
success, but in the tcpm WG there are discussions about an extension for
including a small amount of data in the SYN+ACK payload. there is no
payload in the SYN packet, which makes it differ from T/TCP significantly
in both opportunities for optimizations and also possibilities for abuse.

this could be used to setup elliptic curve cryptography in a DNS exchange
quicker than the standard 3-way handshake would allow. it could be used
to send a previously established, cached cookie between servers such
that only the first connection in a given window incurs the time required
by a full handshake (where the 4th packet [<- ACK+data] contains the
cookie & and response from the request in the 3rd packet [-> ACK+data]).

i haven't given much thought to this, so this is not a formal proposal
to go down this road nor have i completely thought out how this could
be used to DNS's advantage. it's just food for thought since you brought
up T/TCP. it'd be better if the requester would be the one to include a
payload earlier, but T/TCP proved the problems within.


-- bill
[ not speaking for my employer, all just random thoughts ]

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From: bill fumerola <billf@mu.org>
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Subject: DNS over SCTP
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On Wed, Aug 20, 2008 at 02:41:41PM +0000, Paul Vixie wrote:
> did RDP (RFC 908, RFC 1151) ever achieve critical mass?

using another transport layer altogether is also a possibility, as you
hint, i don't believe RDP ever had much traction. however, SCTP could
be used to setup a multiplexed connection such that control messages
(broadly defined for now) are sent down through one stream and other
streams could be used for queries/responses. the advantages of UDP's
unordered delivery and message boundaries still can be realized while
gaining the advantage's of TCP's reliability, path MTU, and congestion
control.

additionally, SCTP has multi-homing support (almost SHIM6-like if i
understand both correctly) which could address the "tcp anycast is broken"
argument by allowing for PA space in addition to PI space to be used to
provide reliability in the face of multihomed servers.

finally, SCTP already contains methods for authenticating chunks on
selected streams using information derived during the setup which can
be based on pre-shared keys - possibly by publishing them in the DNS
tree itself (TKEY or similar).

i don't claim to be an expert on DNS, SCTP, or cryptography. however,
from what i read, SCTP certainly fits the bill for the requirements i've
seen floating around. stub resolvers could remain as-is and SCTP could
be used as transport soley between recursive and authoritative.  this
work would be the long view while EDNS PING, DNSSEC, and other
countermeasures to the problems at hand are deployed.

disadvantages to SCTP could include: lack of hardware accelleration in
network cards for the transport, the virgin territory of SCTP
implementations deployed, the existing problems of using a transport
with more state than UDP, lack of familiarity amongst operators of SCTP,
and a lack of widespread support for SCTP in both host and routing
operating systems.

-- bill
[ not speaking for my employer, all just random thoughts ]

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(note, these are taken from some thought I've been writing down in our  
group blog, http://blog.icir.org/2008/08/entropy-blind-attacks-and-dns.html 
, comments greatly appreciated).


On Aug 18, 2008, at 1:06 PM, George Barwood wrote:
> (2)  When checking a response, a good model is to estimate the  
> number of bits of entropy (random bits) that have been retained from  
> the original request ( I will refer to this as the Confidence value ).
>
> The port number entropy should be discounted if the program may be  
> behind a NAT device, unless it is known that the device preserves  
> port randomization. I think this might be mentioned somewhere in the  
> standard.

The question is, how to KNOW this.

We have a test server for a bunch of tests, at a temporary location as  
part of a larger project.

One of the tests, port.{anything}.nettest.icir.org

will return the port number in the lower 16 bits of the IP address.

My belief is that there should be an official server with this  
property.  Thus resolvers can query the server a few times on startup  
to know if the port number is preserved.  [1]

Yes, its a software "phone home", but given how much evil stuff you  
can hide in code, you have to trust the code for your DNS resolver  
anyway, so whats so bad about having to trust its phone-home to check  
for network properties?

> (3) A possible implementation technique is to maintain a Confidence  
> field for each cache entry.
> When processing a response, the Confidence value computed in (2) can  
> be added in when an exactly matching cache element ( normally with  
> expired TTL ) is found.

Here is my thought on entropy based defenses against blind attacks.   
Pardon if all of this has been hashed out already, but even in that  
case its probably worth remembering:



There are two classes (when viewed from one perspective) of DNS  
attacks: transactional attacks (where the attacker "wins" if the  
transaction is corrupted) or cache attacks (where the attacker "wins"  
if the cache is corrupted.)

There are very few blind attack scenarios which are transactional [2],  
but they do exist, and defenses can vary on how much they protect  
transactions vs the cache.


I don't like the idea of individual confidence, however.  I prefer a  
simpler model of a global entropy budget and a global paranoia level,  
its far simpler and easier to manage.


And for such an entropy budget, 40b is probably sufficient to protect  
the cache.  Here's why.


The probability of success, for attacking a resolver with K bits of  
entropy in the request with N tries is:

P = 1 - (1-2^-k)^N    (Namely, the probability of ALL failing is  
(1-2^k)^N, which means the probability of at least one success P = 1- 
(1-2^k)^N)

To put in some concrete numbers: assume an attempt is 100B of data,  
and the attacker is happy with a roughly 1.5% chance of success.

With k = 16 and N = 1000, P = .015 and it took 10 KB of data.  Owch.

With k = 32 and N = 7e7, P = .016 and it took 7 GB of data.  Not bad.

With k = 40 and N = 2e10, P = .018 and it took 2 TB of data.  HA!


And remember, this is a "bear race": The resolver doesn't have to be  
100% bulletproof, it just has to be strong enough that it is not  
economically viable to attack.  A botnet which can spew 2 TB of  
spoofed data is a pretty valuable resource, who wants to waste it for  
a <2% chance of success?



Failed attempts, however, are easily detectible, as many have pointed  
out:  Any response which mismatches on the entropy (EG, to a different  
port, with a different transaction ID, which doesn't just all-lower or  
all-upper an 0x20 response, but uses a different captialization) is an  
unsolicited response, caused by either a buggy server (they exist but  
are reasonably rare) or an attack.


More importantly, it appears plausible to use this property to set a  
"Maximum P of the cache having a corrupt entry" in practice, and  
RESPOND to it.

Choose a good P, say .0001 (or, put it this way, a .01% chance that  
there exists one or more bad cache entries), plus your minimum entropy  
budget for transaction, and maintain a single global count of  
unsolicited responses.

Now if the number of unsolicited responses is enough that P is over  
your threshold of paranoia, just flush the ENTIRE cache, accept the  
latency hit and extra traffic until you repopulate, and be happy.

For low K (eg 16b), you fail.  Don't bother.  If k is 16b, you are  
dead anyway.

And for a moderate k, this isn't that good.  EG, with P being approx . 
0001 (moderately paranoid),

With k = 32, N would be roughly 5e5, or 50 MB of data.  If your cache  
has 1M entries, this would require refetching, say, 500 MB of data.   
So this, when used as a DOS, would be a roughly 10x amplification, not  
great, but not horrible.  How paranoid are you?


But with a high k, say 40 bits, it IS good.  Lets set P to be approx . 
00001 (or a .001% chance of a single bad cache entry, high paranoia).

With k = 40, N would be roughly 1e7, or 1 GB of data.  So if this is a  
"DOS", it isn't: there's negative amplification. If an attacker needs  
to send 1 GB of data at my resolver, to cause it to flush its cache  
and refetch 500 MB of data, or to have a .001% chance of inserting a  
bad cache entry, he's welcome to it!  Bots are valuable, and the ROI  
for such an attack can only be described as pathetic.

But at the same time, this says "Don't bother trying to get the  
entropy above 40 bits".  40 bits can leave you such a comfortable  
margin that you don't need to get above it, even if you are paranoid  
about flushing the cache when you think you might have been attacked.


And 40 bits is easily achiveable without duplication for most queries  
when not NATed.

Random TXID: 			16b
Random port: 			13b
Random selection of resolver:	 2b
Random caps (www.foo.com):	 9b
-----------------------------------
				40b

And you can know when you are generating the query if you meet your  
entropy budget or not (assuming fallback of rerequest on 0x20 failure  
as "all lower" or "all upper", and checking for NAT), so you can just  
look at your entropy budget and decide if you need to do something more.


And "something more" being duplication has an interesting property,  
depending on your behavior, that needs to be remembered.

If your policy is "send two queries (same query, different entropy  
values), return first, cache only on agreement":

Ups cache entry by nearly double: the attacker must match both from  
the same query to succeed in poisoning the cache.  So if your initial  
entropy is K bits, it should make it 2K-1 bits of entropy.  Cool  
beans.  For protecting the cache, NATs don't matter if you know you  
are behind one.

REDUCES transactional entropy by 1 bit: the attacker gains a minor  
birthday advantage, so if your initial entropy is K bits, it makes  
transactional entropy K-1 bits.  Uhhh, how serious do you consider  
transaction attacks vs cache attacks? It gets down into the question  
on the footnote 2.

But there are some anomalous servers, which for the same repeated  
query will return different values.  With this policy an anomalous  
server which returns different values for the same query will not be  
cached yet will be resolved by the client.  Cool beans: You punish  
them with more load, but their results still work.


If your policy is "send two queries, return and cache only on  
agreement":

You still get the great increase in cache entropy, you increase  
transactional entropy (yay), but the anomalous servers don't work  
anymore at all (boo?).




So with duplication to increase entropy, although it works great to  
protect the cache, you have to decide how you want to protect  
transactions:  Do you want to decrease the transactional entropy  
slightly, or do you want to not resolve these anomalous servers?




(Acknowledgements:  This discussion was shaped by a lot of discussions  
with many individuals, including David Dagon, Robin Sommer, Wouter  
Wijngaards, Mattias Valintin, Dan Kaminski, and I'm sure I'm  
forgetting a few others).



[1] Although many people consider nat "Malicious", there is no reason  
for a nat or firewall to special case such a query, so the value can  
be trusted.  Because if a NAT or firewall DID special case such a  
query, it should be considered an agressive Man-in-the-Middle attacker  
anyway, and nothing short of DNSSEC works for that.

[2] The only scenario I can determine where a blind TRANSACTIONAL  
attack is useful (vs a blind cache attack) is cookie/authentication  
credential stealing from a site with insecure cookie handling.

Eg, login.yahoo.com holds Yahoo's global session cookie, which is  
needed to log into yahoo mail.

1)  Notify the attacker (by doing a DNS lookup by opening an iframe on  
a sub-domain of the attacker's control)

2)  Open an iFrame to login.yahoo.com, while the attacker  
simultaneously launches a traditional blind poisoning attack for  
login.yahoo.akadns.net.

3)  Observe that cookie policy is "specific": cookies for  
login.yahoo.com are returned for 1.login.yahoo.com, 2.login.yahoo.com,  
etc, so you can open up a gazillion iframes, each for different  
variants, getting the "run N races and win one" property but for a  
transactional attack.

However, notice that for a blind transactional attack to work against  
an HTTP site, the site is also trivially vulnerable to Mike Perry's  
attack using TCP packet injection, so how much protection is really  
necessary to build into the DNS transaction (vs the cache) for  
software thats already b0rken?



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From: bert hubert <bert.hubert@netherlabs.nl>
To: Paul Vixie <vixie@isc.org>
Cc: namedroppers@ops.ietf.org
Subject: Re: SCTP (and DCCP)
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On Thu, Aug 21, 2008 at 04:32:06PM +0000, Paul Vixie wrote:
> know i said that in the MODA proceedings, but i've since then been proved
> right, but now we've seen a 10-hour attack against the only mitigation
> we've got. 

It is not the only mitigation.

Even very simple countermeasures foil the '10 hour attack' and turn it into
a '100 year attack' (on average), or perhaps even a '500 year attack'.

It turns out that detecting a spoofing attempt in progress is easy, and that
simple agile behaviour makes attacks infeasible or at least very uninteresting.

It is not cool and revolutionary though.. But the upside is that it does not
require deprecating DNS over TCP, nor does it require moving DNS to SCTP or
DCCP other exciting new protocols.

	Bert

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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From: Mohsen Souissi <mohsen.souissi@nic.fr>
To: Paul Vixie <vixie@vix.com>
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Subject: Re: deprecating dangerous bit patterns and non-TC non-AXFR
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 On 20 Aug, Paul Vixie wrote:

 | i worry about
 | <http://tools.ietf.org/html/draft-heffner-frag-harmful-02> and
 | <http://tools.ietf.org/html/rfc4963>.  i mention the
 | earlier-than-final draft because its title was "Fragmentation
 | Considered Very Harmful" which was a play on WRL-87-3
 | "Fragmentation Considered Harmful" (Kent and Mogul, DECWRL 1987).
 | BIND has had to implement all kinds of fallbacks in its EDNS0
 | support due to firewalls that don't allow fragments or which do the
 | wrong thing with them.  i am therefore not as convinced today as i
 | was in RFC 2671 that fragmentation is a reasonable way to expand
 | the DNS message size beyond 512 octets.

==> Hmm, I can see. Otoh, nobody could imagine at that time (and even
10 years ago) how the network-layer would become complex and its
components (often) misbehaving (magic combination of NATs, Firewalls, Load
Balancers...). So don't blame yourself ;-)


[...]

 | there is work going on in this WG to make EDNS0 mandatory.  that will have
 | an impact far broader than what we say to eachother in the forum itself.
 | as you yourself point out:
 | 
 | > 2) It is directly related to the discussion which took place on dnsext ml
 | > while editing dns-protocol-profile:
 | > http://www.ops.ietf.org/lists/namedroppers/namedroppers.2008/msg00037.html
 | > (see section 4.2.2).
 | > 
 | > The I-D expired on Jul 22nd, a copy is available here:
 | > http://ietfreport.isoc.org/idref/draft-ietf-dnsext-dns-protocol-profile/
 | > 
 | > This I-D should be recycled in the near future as I understood from last
 | > dnsext session @ IETF. And then, the result of the current debate may be
 | > helpful for people in charge of editing next version
 | > dns-protocol-profile...
 | > 
 | > Mohsen.
 | 
 | it's possible that you (mohsen) should volunteer to the WG chairs to help
 | edit that document, since i believe its current authors are overcommitted.

==> During IETF@Dublin, Ólafur discussed that matter with the editors
(and maybe others). Stéphane Bortzmeyer (a colleague of mine) was
among them and committed with some others to taking again that task
before next IETF. Hope it will efficiently move forward by then.

Mohsen.


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> It is not the only mitigation.

nominum, powerdns, and unbound are probably doing more than port
randomization.  perhaps you can all three explain what you're doing, in
detail, so that the WG can decide whether those are reasonable things to
recommend to the rest of the community.

(for BIND, ISC explicitly decided not to implement anything experimental,
not even dns-0x20, during the six month period during which patches had to
be prepared in secrecy.  we'd like to do more, but we don't want to get too
far ahead of the WG's thinking on this.)

> It is not cool and revolutionary though.. But the upside is that it does
> not require deprecating DNS over TCP, nor does it require moving DNS to
> SCTP or DCCP other exciting new protocols.

do tell.

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From owner-namedroppers@ops.ietf.org  Thu Aug 21 12:56:58 2008
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On Aug 21, 2008, at 10:30 AM, Paul Vixie wrote:

>> It is not the only mitigation.
>
> nominum, powerdns, and unbound are probably doing more than port
> randomization.  perhaps you can all three explain what you're doing,  
> in
> detail, so that the WG can decide whether those are reasonable  
> things to
> recommend to the rest of the community.

Note, I'm not a DNS developer.  However, I have been looking at these  
from the IDS viewpoint and attacker viewpoint, and also been  
corresponding with one of the Unbound developers (so a lot of what I'm  
going to say is influenced by that discussion as well, full acks in my  
previous mail).

But I believe there are several mitigations, all of them which are  
very powerful, beyond just increasing entropy, that should at least be  
considered.

So how do you think about mitigating things when you think like the  
IDS crowd does?


First, develop a taxonomy of various properties of attacks.

Blind vs Aware attacks:  Does the attacker have to guess any entropy  
or is it known to the attacker?

Transparent vs Blocking attacks:  Is the attacker unable to squelch  
the legitimate response or will the legitimate response be blocked?

Direct Record vs Glue: The resolver's query is in the form "X is ?".   
Is the attacker's desire to get "X is EVIL", or is the attacker's  
desire to get "SOMETHING_ELSE is EVIL" to be accepted (where  
SOMETHING_EVIL is ANYTHING beyond the direct answer of "X is Y", it  
could be an additional record, an authority record, something like "X  
CNAME TARGET,TARGET A EVIL")?

Transaction vs Cache:  Does the attacker desire that the eventual  
victim act on the transaction, or is it necessary for the victim's  
resolver to cache the response?



Then look at how attackers fit in the taxonomy.  A packet injector is  
"Aware and transparent", while a MitM is "Aware and blocking".  "Aware  
+ blocking" == game over short of crypto.  But you know that.

In particular, Yahoo cookie hijacking (as described in a previous  
message) is a blind, direct record, transaction attack, that  
nonetheless has a "race until win" property, although it takes  
advantage of interlocking weaknesses (when the browser sends cookies,  
how Yahoo handles cookies) in order to gain "Run until win".

Kaminski attacks are blind, glue, cache attacks:  The actual response  
is meaningless, and it is that they are a glue attack is what enables  
it to be "Run until Win" rather than "Run every TTL until Win" which  
doesn't reduce the packet count required but does greatly reduce the  
time involved.

(is there ANY kaminski variant that has "X is Y" as the only response  
the attacker wants to cache?  I don't believe so, because that's old- 
school cache poisoning.)


Blind attacks like this MAY be transparent, or they MAY be enough of a  
DOS to be blocking.  It depends on how much hostility you want to  
direct at your victim's network.



This taxonomy can then guide defenses:

Entropy increases (per previous post) (port randomization, dns-0x20,  
randomly selecting authority (per unbound)) protects against blind  
attacks with probabilistic bounds.  40 bits of entropy gives you good  
comfort, even when paranoid like me.

Duplication acts to increase entropy for the cache by nearly 2x, but  
either:
a) Decreases it for transactions (by 1 bit) while still resolving  
anomalous servers
b) Increases it for transactions (by nearly 2x) while preventing  
anomalous servers from resolving.

So pick your tradeoff if you need to duplicate to add entropy: do you  
want to allow blind transactional attacks and anomalous servers, or  
block blind transaction attacks and anomalous servers.


Yet entropy is also a "bear race": bots are valuable resources, so you  
don't need 100% protection, just enough protection that an attack is  
economically unfeasible.  40 bits and even paranoid me is happy.



Blind attacks can also be trivially detected, both by the IDS and by  
the DNS resolver: they generate responses that don't match requests,  
so you can say "I KNOW I am under attack" and "do something", which I  
BELIEVE allows you to say "the probability of their being one or more  
poisoned entries in my cache is less than P" by voiding the cache  
completely when it is greater than P (see the previous discussion on  
why you should be able to set P really low and not have this enable a  
DOS if you have sufficient entropy)



Transparent attacks can be detected as well.  They generate two or  
more responses for the SAME request but with different values, within  
the same timeout.  A preliminary IDS based study shows that this is  
VERY rare (1 server seen at ICSI, 30 seen at Ohio State, under a week+  
of traffic), so it is a very low false-positive situation.

The stateholding to detect such an attack is reasonable but not  
trivial.  Assume 100k active outbound requests/second.  With 1KB/ 
record stateholding, and a 3 second timeout, this is 300MB of  
stateholding to detect transparent attacks at a massively busy resolver.

Transparent transaction attacks can be detected in this manner.  And  
the detection of the attack could be forwarded to the client as well:  
take the second result, set the TTL to 1s, and forward it to the  
client to indicate a mismatch, allowing the client to detect the same  
thing the resolver did (plus packet injectors on the local network).

Transparent cache attacks can be mitigated, not just detected.  When a  
transparent attack is detected, either UNDO or INVALIDATE any cache  
changes caused by the first response.  It gets to be a maze of  
pointers, but I THINK this can be done "cleanly" (constant time/ 
request for all work).

Thus someone able to directly observe all the DNS traffic from the  
resolver and inject packets is both detectible (transparent  
transaction attacks are detected) and can only affect the results  
while in-path (transparent cache attacks are mitigated).

Likewise, unless a blind attack generates enough traffic that the  
legitimate response is blocked, the blind attack can't affect the  
cache, and is detected for the transaction.

The effect on anomalous servers which trigger this (which, as I  
mentioned, are few) is

a:  Their results are NEVER cached.
b:  If the eventual client software is suitably paranoid, transactions  
won't be conducted.



"blind direct cache" attacks (old school cache poisoning) have a "Run  
every TTL until Win" property, which is good.  You make the  
probability of winning low (through entropy), AND you make it so you  
can't run often, and you are happy.  Lets keep it that way.

The only case where a "blind direct cache" attack on a single name is  
"run until win" is if the legitimate response either doesn't return or  
returns an error.

Thus a question:  Should error lookups for name X also have an  
implicit TTL (of say, 1 minute?) in the resolver.




And there APPEARS to be policies on glue which mitigate the glue  
portion of a "blind glue cache" attack, without increasing the power  
of an "aware glue cache" attack.  (Glue is somewhat "out of bailywick"  
for me, pun intended, but...)

The blind glue attacks gain much of its power from "Run until Win" on  
the race condition, rather than "Run every TTL until Win".  Run until  
win does not reduce the number of packets required, but greatly  
reduces the amount of TIME required.

If the policy on all the additional garbage (INCLUDING the information  
about the authoritative nameservers, what all the CNAMEs point to, etc  
etc etc etc etc.  Yes, I mean EVERYTHING other than 'X is Y'!) is to  
"Never cache, only use for the current transaction.  PERIOD.", this  
completely blocks the "aware glue cache" attacks as far as I know, as  
I have yet to see a kaminski variant which is:

"Cause server to request X, response with 'X is Y'"

Simply because the race for any given X can only be run once every TTL  
(excluding failures, as mentioned previously), so you're back to the  
defender's happy place of "run every TTL until win".


Of course, such a glue policy would cause a huge efficiency hit, as  
certain things (like who's the authoritative server for .com) never  
get cached.  OOps.

However, if the resolver takes all the additional garbage it would  
have cached and does separate background lookups to validate each  
piece thats not in the cache "(authority for .com is?  A record for  
a.gtld-servers.net is?, A record for b.gtld-servers.net is? ...)", now  
all the subsequent lookups will run exactly as we would have expected  
without this policy change, including cache behavior.

Yet at the same time, it should defang all "blind glue cache" attacks,  
because instead of being "run until win", 'win' becomes simply the  
start of ANOTHER race that both has an unpredictable start AND can  
only be "run every TTL until win", because the result gets cached.

I also THINK this subsumes all the bailywick checking business which  
just gives me a headache.

And it doesn't increase the power of "aware glue cache" attacks, it  
just means the attacker must send a few more packets.



This should have two effects beyond the attacker.  If the authority is  
b0rken, and doesn't return things like the ns query, it will not be  
cached but will still be reachable.  (ALL the crud is still respected  
within the context of the current transaction only.  It will just  
never be cached).

And it increases overall load on the DNS authorities, by an "I'm not  
sure how much" level (remember, the stuff being asked for should cache  
really well).  It should be possible, however, to "given a trace piped  
through Bro, estimate the # of additional queries which would be  
generated if the authoritative servers aren't b0rken" if those on the  
list would think it valuable.



And there are also projects to revalidate caches as well, eg http://www.onzra.com/cacheaudit.html 
, which attempts to mitigate the duration of all cache attacks where  
the auditor is not under the same attack path as the resolver.




Thus also, layers of defenses are important.

Entropy mitigates blind attacks.

Mismatch detection detects (on transaction)/mitigates (on cache) aware  
attacks, even against packet injectors.

"Cache nothing I did not actually ask for, period" looks like it  
mitigates blind-glue attacks on the cache.

Auditing can detect cache attacks.

This is why this IDS person believes there are many options for  
mitigation, far more than just port randomization and 0x20, and they  
all should at least be considered and understood.



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From owner-namedroppers@ops.ietf.org  Thu Aug 21 13:18:50 2008
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From: bert hubert <bert.hubert@netherlabs.nl>
To: Paul Vixie <vixie@isc.org>
Cc: namedroppers@ops.ietf.org
Subject: Agile countermeasures
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On Thu, Aug 21, 2008 at 05:30:36PM +0000, Paul Vixie wrote:
> > It is not the only mitigation.
> 
> nominum, powerdns, and unbound are probably doing more than port
> randomization.  perhaps you can all three explain what you're doing, in
> detail, so that the WG can decide whether those are reasonable things to
> recommend to the rest of the community.

That sounds like a very fine initiative. I've been holding back because
'thinking out loud' between implementors might not be DNSEXT-material.
Perhaps it is also something that might benefit from some privacy.

The basic ideas are probably good to get out in the open, if only to create
some documented prior art. I'd hate for someone to patent an effective
countermeasure. Note well indeed.

The basic premise is that it is easy to detect any targeted attack, even a
'kaminsky-style' attack, as outlined in
http://www.ops.ietf.org/lists/namedroppers/namedroppers.2008/msg01213.html

The referenced post is light on what to do if an attack on a zone apex is
detected. (forgive me my weak DNS terminology, the post outlines what I
mean)

Some ideas below - these are the things I've researched enough to make
statements about, some other ideas are still cooking.

A number of things appear to work some of the time:

1) open up a semi-persistent TCP channel and funnel all subsequent queries
for that zone apex and that server over it. This incurs syn, synack, ack,
fin, finack ack, but as we're on the receiving end of thousands of queries
by that time, this overhead is not significant. Keep the channel alive until
the responder disconnects, and reopen it. Fails on hosts which don't do TCP.
If attempts to outlaw DNS over TCP succeed, this percentage might rise.

Conversely, if we reaffirm TCP's first class citizen status for DNS, and
"clarify" the timout rules, this option becomes more succesful.

2) Repeat queries n times (fails on a number of important content
distribution networks, am in talks with those)

3) DNS-0x20 - although that doesn't protect the vital and scary . and COM
records from numerical kaminsky attacks.

What always works is:

4) Stop accepting new data for the attacked zone apex and everything beneath
it. 

This has the downside that over time, the TTL of the bonafide data expires,
turning a spoof into a DoS.

A more advanced way is:

5) Stop accepting new data below the attacked apex, but also stop expiring
it.

This last option opens up a subtle and expensive DoS opportunity to keep old
data alive, and to prevent new data from entering the cache. 

Some unexpected things that work:

6) Keep track of unresponsive servers, and stop sending them queries. It
turns out to be very hard to dose a DoS such that you overwhelm the correct
answers, but still allow most of them to get through.

My own implementation is lucky in this respect - I never intended this as an
anti-spoofing measure, but in my own experiments it is very hard not to
trigger this protection, and still maintain adequate spoofing bandwidth.

7) Don't have too much effective bandwidth. It turns out that it does not
really matter how much bandwidth an attacker can generate. What matters is
how much a receiving nameserver can process. This is limited by its incoming
bandwidth, plus the performance of its implementation.

What might work in the nearish future:

8) EDNS PING. Currently supported by 2 (two) hosts on the internet. David
Ulevitch and I will be releasing patches for BIND 9, NSD and DJBDNS, plus
PowerDNS will of course support it.

It turns out that you discover the things that work and that don't work by
actually implementing the countermeasures and seeing what happens. The naive
'drop back to TCP' for example proved to be an instant DoS on the authentic
authoritative servers.

>From this came the 'semi-persistent TCP channel', which works very well.

The discovery that keeping track of servers that generate timeouts is an
effective protection also came out of attempts to spoof PowerDNS.

I'm pretty sure that we'll discover ever better techniques as time
progresses.

For now the best recipe appears to be a mix of 1, 2, 3 and 8 and use 5 if
those fail.

The best an attacker can then do is keep a limited number of domains (that
don't do TCP and that fail the 'try n times'-test) from receiving new data.

I realise the agile techniques mentioned above are not very 'clean'. But in
the end, it is results that matter. The challenge is to have these
countermeasures not turn into new DoS-vectors (as noted by David Conrad),
but otherwise all real world engineering has its dirty spots.

	Bert

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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From:	 JINMEI Tatuya / =?ISO-2022-JP?B?GyRCP0BMQEMjOkgbKEI=?=
 <Jinmei_Tatuya@isc.org>
To:	 bert hubert <bert.hubert@netherlabs.nl>
Cc:	 Paul Vixie <vixie@isc.org>,
	 namedroppers@ops.ietf.org
Subject: how to spoof . by Kaminsky's method (Re: Agile countermeasures)
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At Thu, 21 Aug 2008 22:12:46 +0200,
bert hubert <bert.hubert@netherlabs.nl> wrote:

> 3) DNS-0x20 - although that doesn't protect the vital and scary . and COM
> records from numerical kaminsky attacks.

This is probably an off-topic for this thread and in any case is
minor, but it's something I've always been wondering, so please let me
ask: how specifically would you spoof . by a "Kaminsky attack"?

---
JINMEI, Tatuya
Internet Systems Consortium, Inc.

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On Aug 21, 2008, at 1:12 PM, bert hubert wrote:
> That sounds like a very fine initiative. I've been holding back  
> because
> 'thinking out loud' between implementors might not be DNSEXT-material.

I think it's namedroppers material, whether or not it's DNSEXT material.

> Perhaps it is also something that might benefit from some privacy.

If your countermeasures depend on people not knowing how they work,  
then they don't work.


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To: "JINMEI Tatuya / ?$B?@L@C#:H" <Jinmei_Tatuya@isc.org>
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Subject: Re: how to spoof . by Kaminsky's method (Re: Agile countermeasures)
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On Thu, Aug 21, 2008 at 02:28:34PM -0700, JINMEI Tatuya / ?$B?@L@C#:H wrote:
> > 3) DNS-0x20 - although that doesn't protect the vital and scary . and COM
> > records from numerical kaminsky attacks.
> 
> This is probably an off-topic for this thread and in any case is
> minor, but it's something I've always been wondering, so please let me
> ask: how specifically would you spoof . by a "Kaminsky attack"?

Jinmei,

Perhaps I'm very mistaken. I think I know more about implementing than I
know about DNS theory.

But this is how I think it works:

Send queries for '1.', '2.', '3.', '4.' etc to a resolver. In the meantime,
blast it with answers for '1.', '2.' etc with new NS records of your choosing
for '.'. Be sure to pick the source address of the nearest root-server.

I don't think . is special in any way in this respect.

	Bert

-- 
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http://netherlabs.nl              Open and Closed source services

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On Thu, Aug 21, 2008 at 02:33:53PM -0700, Ted Lemon wrote:
> >Perhaps it is also something that might benefit from some privacy.
> 
> If your countermeasures depend on people not knowing how they work,  
> then they don't work.

Well - I was basically saying this on behalf of companies that might have a
hard time disclosing their (internal) deliberations, or perhaps intellectual
property.

It is not about keeping things ultimately secret.

I wouldn't be able to anyhow - "the source is out there".

	Bert

-- 
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From:	 JINMEI Tatuya / =?ISO-2022-JP?B?GyRCP0BMQEMjOkgbKEI=?=
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At Thu, 21 Aug 2008 23:35:12 +0200,
bert hubert <bert.hubert@netherlabs.nl> wrote:

> > This is probably an off-topic for this thread and in any case is
> > minor, but it's something I've always been wondering, so please let me
> > ask: how specifically would you spoof . by a "Kaminsky attack"?

> Perhaps I'm very mistaken. I think I know more about implementing than I
> know about DNS theory.
> 
> But this is how I think it works:
> 
> Send queries for '1.', '2.', '3.', '4.' etc to a resolver. In the meantime,
> blast it with answers for '1.', '2.' etc with new NS records of your choosing
> for '.'. Be sure to pick the source address of the nearest root-server.

So, do you mean something like this?

- the attacker (somehow) force the recursive server to send a query
  for (e.g.) '1. IN AAAA'
- then the attacker sends a forged response as follows:
  question: 1. IN AAAA
  authority: . IN NS evil.example.
  additional: evil.example. AAAA 2001:db8::1
- the recursive server replaces the forged NS RRset with the
  legitimate one:
  . IN NS [a-m].root-servers.net.

---
JINMEI, Tatuya
Internet Systems Consortium, Inc.

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On Thu, Aug 21, 2008 at 02:55:11PM -0700, JINMEI Tatuya / ?$B?@L@C#:H wrote:
> - the recursive server replaces the forged NS RRset with the
>   legitimate one:
>   . IN NS [a-m].root-servers.net.

Well, you could do that - hardcode the list of root-servers. Is that what
people do?

	Bert

-- 
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From:	 JINMEI Tatuya / =?ISO-2022-JP?B?GyRCP0BMQEMjOkgbKEI=?=
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Subject: Re: how to spoof . by Kaminsky's method (Re: Agile countermeasures)
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At Fri, 22 Aug 2008 00:04:38 +0200,
bert hubert <bert.hubert@netherlabs.nl> wrote:

> > - the recursive server replaces the forged NS RRset with the
> >   legitimate one:
> >   . IN NS [a-m].root-servers.net.
> 
> Well, you could do that - hardcode the list of root-servers. Is that what
> people do?

Oops, I meant:

- the recursive server replaces the legitimate NS RRset for .
  (which is normally) . IN NS [a-m].root-servers.net.
  with the forged NS RRset

Is this what you had in your mind?

---
JINMEI, Tatuya
Internet Systems Consortium, Inc.

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Subject: Re: how to spoof . by Kaminsky's method (Re: Agile countermeasures)
Date: Thu, 21 Aug 2008 15:16:33 -0700
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On Aug 21, 2008, at 2:28 PM, JINMEI Tatuya / =E7=A5=9E=E6=98=8E=E9=81=94=E5=
=93=89 wrote:

> At Thu, 21 Aug 2008 22:12:46 +0200,
> bert hubert <bert.hubert@netherlabs.nl> wrote:
>
>> 3) DNS-0x20 - although that doesn't protect the vital and scary . =20
>> and COM
>> records from numerical kaminsky attacks.
>
> This is probably an off-topic for this thread and in any case is
> minor, but it's something I've always been wondering, so please let me
> ask: how specifically would you spoof . by a "Kaminsky attack"?

A:  Its not off topic.

B:  Its actually fun to explain.  So here goes:


When a DNS resolver asks for a mapping of the form "X is WHAT?" and =20
gets a reply back from the authoritative server that "X is SOMETHING", =20=

there is a lot of other information returned by the authoritative =20
server, including things like "Y is Z" and "Authorities for mydomain =20
are R, S, T at these IP addreses" and "Oh by the way, =20
adds.mydomain.com is this IP address".

These records are all potentially needed to complete the current =20
transaction, but effectively all DNS resolvers will, under some =20
conditions, cache this additional data, so subsequently the resolver =20
will not have to ask, but can just check out what it has already for =20
various purposes.  (This is the whole "Bailywick" checking business).


This interacts, umm, badly, with the "blind" attack.

The classic blind attack is: I cause the DNS resolver to request 'X is =20=

WHAT?', and send a bunch of forged replies that look like they are =20
coming from the legitimate authority in the form 'X is MY_EVIL_RESULT'.

If I get lucky (and select the same transaction ID, port number, etc), =20=

the DNS server caches my response and for now until my TTL expires, =20
the DNS resolver will always believe that "X is MY_EVIL_RESULT", and =20
anyone else who asks it will get 'X is MY_EVIL_RESULT'

And its pretty easy to get lucky unless there are randomized ports or =20=

other entropy sources, because the transaction ID is 16 bits.  Thus =20
for just a single try, if I try 1000 responses, the odds of success =20
are roughly 1.5%.  Decent but not great odds.

However, if I failed, the DNS resolver got back 'X is GOOD' from the =20
real authority, and will not do another request until the TTL expires, =20=

which can be hours (or days).  This makes the attacker unhappy.


The kaminski attack is a surprisingly minor variant.  The attacker =20
causes the DNS resolver to request 'SOMETHING_I_DONT_CARE is WHAT?", =20
and sends a bunch of replies in the form of 'SOMETHING_I_DONT_CARE is =20=

WHATEVER, oh, and by the way, X is MY_EVIL_RESULT'.  Or any one of a =20
bazillion variants of this form.

If the attacker gets lucky, the name server now believes 'X is =20
MY_EVIL_RESULT'

Now the attacker, if he fails, can try again immediately by asking for =20=

'SOMETHING_ELSE_I_DONT_CARE_ABOUT', because thats not in the cache and =20=

causes the DNS resolver to try again.

Thus it changes the threat model from "Try once every X hours" to =20
"Just keep trying until I succeed".  So something that might have =20
required days of waiting and 20,000 packets now requires just 20,000 =20
packets, no waiting!


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On Aug 21, 2008, at 2:52 PM, bert hubert wrote:
> Well - I was basically saying this on behalf of companies that might  
> have a
> hard time disclosing their (internal) deliberations, or perhaps  
> intellectual
> property.

Understood.   But in fact it's probably better that discussions like  
that not percolate out into the greater IETF community, since they  
might affect determinations about prior art (speaking as one who has  
been burned, albeit mildly, by this in the past).


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Subject: Re: how to spoof . by Kaminsky's method (Re: Agile countermeasures)
Date: Thu, 21 Aug 2008 15:19:03 -0700
References: <200808211532.m7LFWJKx046469@givry.fdupont.fr> <40391.1219336326@nsa.vix.com> <20080821170545.GB14116@outpost.ds9a.nl> <49938.1219339836@nsa.vix.com> <20080821201246.GE14116@outpost.ds9a.nl> <m2myj6vz0d.wl%Jinmei_Tatuya@isc.org> <13AD68BF-5F0E-4695-B2F5-4D97F08D3504@icsi.berkeley.edu>
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>
> On Aug 21, 2008, at 2:28 PM, JINMEI Tatuya / =E7=A5=9E=E6=98=8E=E9=81=94=
=E5=93=89 wrote:
>
>> At Thu, 21 Aug 2008 22:12:46 +0200,
>> bert hubert <bert.hubert@netherlabs.nl> wrote:
>>
>>> 3) DNS-0x20 - although that doesn't protect the vital and scary . =20=

>>> and COM
>>> records from numerical kaminsky attacks.
>>
>> This is probably an off-topic for this thread and in any case is
>> minor, but it's something I've always been wondering, so please let =20=

>> me
>> ask: how specifically would you spoof . by a "Kaminsky attack"?
>
> A:  Its not off topic.
>
> B:  Its actually fun to explain.  So here goes:

Err, me bad, missed the fundimental addition of how you spoof .


You make your requests for

B123.com
B124.com
B125.com

And in the authority field, you give a new authority for .com

Now you only have 4 bits of entropy for 0x20.


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From:	 JINMEI Tatuya / =?ISO-2022-JP?B?GyRCP0BMQEMjOkgbKEI=?=
 <Jinmei_Tatuya@isc.org>
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Subject: Re: how to spoof . by Kaminsky's method (Re: Agile countermeasures)
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At Thu, 21 Aug 2008 15:16:33 -0700,
Nicholas Weaver <nweaver@ICSI.Berkeley.EDU> wrote:

> > This is probably an off-topic for this thread and in any case is
> > minor, but it's something I've always been wondering, so please let me
> > ask: how specifically would you spoof . by a "Kaminsky attack"?
> 
> A:  Its not off topic.
> 
> B:  Its actually fun to explain.  So here goes:

Thanks for the lecture, but I believe I'm one of the people in the
world who know how the Kaminsky attack generally works very well:-)

My question was how specifically it works for ".".  I'd like to see a
specific sequence of question, forged response, resulting poisoned
cache entry for this specific target.

---
JINMEI, Tatuya
Internet Systems Consortium, Inc.

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From owner-namedroppers@ops.ietf.org  Thu Aug 21 15:46:50 2008
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Subject: Re: how to spoof . by Kaminsky's method (Re: Agile countermeasures)
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Again, apologies for my previously stupid reply.

However, it makes me wonder:

What are the conditions where various DNS resolver implementations  
will REPLACE a cache entry vs ADD a cache entry based on the reply.

EG, the cache has the RRset
.com NS is {a-m}.gtld-servers.net

living in the cache effectively forever.

What conditions in an authoritative reply will cause this to be  
evicted/replaced with new information?


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From:	 JINMEI Tatuya / =?ISO-2022-JP?B?GyRCP0BMQEMjOkgbKEI=?=
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At Thu, 21 Aug 2008 15:19:03 -0700,
Nicholas Weaver <nweaver@ICSI.Berkeley.EDU> wrote:

> Err, me bad, missed the fundimental addition of how you spoof .
> 
> You make your requests for
> 
> B123.com
> B124.com
> B125.com
> 
> And in the authority field, you give a new authority for .com
> 
> Now you only have 4 bits of entropy for 0x20.

I know this works (btw the attacker would even omit 'B', which should
also work).  I didn't ask that.   My question was very specifically
about ".".

Speaking about "com", I think "doesn't protect" in the following
sentence

: 3) DNS-0x20 - although that doesn't protect the vital and scary . and COM
: records from numerical kaminsky attacks.

is not very accurate.  0x20 does provide protection for COM, but only
with a small bit of entropy (3 bits).  It's of course not sufficient,
but my understanding is that 0x20 is not intended to be a single
complete counter measure in the first place (i.e. it's expected to be
used with other source of entropy), so I'd say even additional 3 bits
are a plus if its cost is reasonable (which I also believe is the
case).

---
JINMEI, Tatuya
Internet Systems Consortium, Inc.

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From owner-namedroppers@ops.ietf.org  Thu Aug 21 16:05:58 2008
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Paul Vixie wrote:

> i see five reasons why SCTP is worth looking at as a primary transport with
> UDP as its fallback.  first, data transfer can take place in the second
> round trip (packets 3 and 4).  second, it has 32-bit ID fields so we could
> go back to fixed port numbers perhaps even fixed+increment on TXID's.
> third, we could mandate EDNS, and with it, we could mandate PING.  fourth,
> SCTP has the idea of "passive" sockets which mean nonquadratic socket pool
> sizes.  fifth, association timeout is handled in the stack not the app.


All the things you talk about are engineering problems which are already 
solved this day.


It's no big issue these days to serve thousands of clients, be it TCP or 
UDP. See [1] for common solutions to the problems, and [2] for 
benchmarks in this area. Nowadays the amount of clients you can serve in 
parallel are only limited by the amount of memory you've got for the 
respective data structures and the performance of the operations which 
are needed to traverse said data structures. RAM is cheap to come by, 
and at least since fefe has pointed out outstanding issues in 
implementations, every major OS should scale fine.

If your application isn't designed for such a task it takes a bit of 
refactoring and a few hours back at the architecture board, but it is 
feasible. Please do not try to design the protocols around your current 
implementation but around current engineering standards.


There's no need to go back to static source ports, the implementations 
which are out there work quite fine. You could also mandate (or 
"SHOULD", in RFC-speak) PING by now with the current UDP/TCP 
infrastructure, it just needs a common vision and a common goal. If you 
get the few major DNS vendors out there to support your cause, 
everything should be fine (tm) in a few years worth (and much earlier 
for those installations were people actually care about DNS).


> i see two gigantic challenges for ANY non-UDP transport: installed base of
> DNS protocol agents; installed base of firewalls and NATs and middleboxes.

Whereas changes in the TCP direction are much easier to come by than 
SCTP/DCCP or any different "newfangled" protocol which installed base is 
tremendeously exceeded by the amount of IPv6 production hosts ;).

Michael

[1] http://www.kegel.com/c10k.html
[2] http://bulk.fefe.de/scalability/

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From owner-namedroppers@ops.ietf.org  Thu Aug 21 16:49:35 2008
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On Aug 21, 2008, at 9:32 AM, Paul Vixie wrote:

>> PS: for SCTP none of the nice features of SCTP has an interest for  
>> the common DNS (i.e., the part which uses UDP when the payload is  
>> not over sized, not AXFR where SCTP makes sense). As these features  
>> are not always for free SCTP has no definitive advantage over TCP  
>> and clearly can't take the place of UDP (for DNS).
>
> i see five reasons why SCTP is worth looking at as a primary  
> transport with UDP as its fallback.  first, data transfer can take  
> place in the second round trip (packets 3 and 4).  second, it has 32- 
> bit ID fields so we could go back to fixed port numbers perhaps even  
> fixed+increment on TXID's. third, we could mandate EDNS, and with  
> it, we could mandate PING.  fourth, SCTP has the idea of "passive"  
> sockets which mean nonquadratic socket pool sizes.  fifth,  
> association timeout is handled in the stack not the app.
>
> i see two gigantic challenges for ANY non-UDP transport: installed  
> base of DNS protocol agents; installed base of firewalls and NATs  
> and middleboxes.

Agreed.  However, there is a fairly sizable install base for SCTP  
since it handles phone switching traffic (SS7), Diameter, respool, and  
MEGACO.  Both Cisco and Juniper support SCTP, and offer SCTP specific  
firewall solutions.  The CRC32c used by SCTP is the same polynomial  
used by iSCSI.  This polynomial has an increased Hamming distance and  
provides about the same error detection rate for Jumbo frames (the  
9000 byte frames desired by JET which includes Abilene (Internet2),  
DREN (DOD), ESnet (DOE), NREN (NASA), as does the IEEE 802.3 CRC for  
its 1518-byte maximum packet size (1500 payload).

SCTP also allows faster setup than TCP, and is fairly immune from  
packet spoofing.  A cookie echo in the handshake holds resource state  
returned by the client attempting to connect.  This approach mitigates  
packet spoofing and is more robust than TCP in dealing with DDoS  
attack.  At some point people will want greater security and  
reliability, and SCTP offers a solution that also avoids the head of  
queue blocking and allows zero copy data placement needed with higher  
bandwidths.  Perhaps just rumors of a new DNS on SCTP would help  
ensure home router vendors update their offering to handle this 8 year  
old IETF IP protocol.  Overcoming the lack of low-end commodity router  
support seems to be a barrier holding back progress.  If not Redmond,  
perhaps Redwood City?

-Doug





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Subject: Re: deprecating dangerous bit patterns and non-TC non-AXFR
References: <g3od3qnuy1.fsf@nsa.vix.com> <82myj85dt4.fsf@mid.bfk.de> <72546.1219243301@nsa.vix.com> <82bpzn3etu.fsf@mid.bfk.de> <81795.1219246023@nsa.vix.com> <20080820172800.GF95996@kerkenna.nic.fr> <56470.1219266519@nsa.vix.com> <20080821171619.GA68008@kerkenna.nic.fr>
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Mohsen Souissi wrote:

>  | i worry about
>  | <http://tools.ietf.org/html/draft-heffner-frag-harmful-02> and
>  | <http://tools.ietf.org/html/rfc4963>.

An inappropriate assumption in them is reassembly timeout of 15 second.

> ==> Hmm, I can see. Otoh, nobody could imagine at that time (and even
> 10 years ago) how the network-layer would become complex and its
> components (often) misbehaving (magic combination of NATs, Firewalls, Load
> Balancers...). So don't blame yourself ;-)

More than 20 years ago when IPv4 was designed, it was considered that
packet transit time can be as long as several or tens of seconds. For
example, TTL of IPv4 is a transit time upper limit measured in seconds.

Then, 15 seconds of reassembly timeout was reasonable.

Today, though TTL could be more than 1 second, which is already
quite unlikely, jitter of packet transit time is a lot less than
1 second that 0.4~0.2 second of reassembly timeout is enough,
which requires several lines of kernel modification.

It solves the reassembly problem, at least for the time being.

						Masataka Ohta


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Subject: Re: deprecating dangerous bit patterns and non-TC non-AXFR
Date: Thu, 21 Aug 2008 18:23:17 -0700
References: <g3od3qnuy1.fsf@nsa.vix.com> <82myj85dt4.fsf@mid.bfk.de> <72546.1219243301@nsa.vix.com> <82bpzn3etu.fsf@mid.bfk.de> <81795.1219246023@nsa.vix.com> <20080820172800.GF95996@kerkenna.nic.fr> <56470.1219266519@nsa.vix.com> <20080821171619.GA68008@kerkenna.nic.fr> <48AE0EA6.5030607@necom830.hpcl.titech.ac.jp>
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On Aug 21, 2008, at 5:56 PM, Masataka Ohta wrote:
> Today, though TTL could be more than 1 second, which is already
> quite unlikely,

I measured ping times to my home server at as much as 40 seconds  
during the most recent IETF meeting.   Arguably, we could describe  
this as an outage.  But unfortunately, there exist networks where  
routers are configured with excessive buffering, or where the layer  
two erroneously provides reliability.   On such networks, when there  
is congestion, long round trip times are actually quite common.


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From owner-namedroppers@ops.ietf.org  Thu Aug 21 19:03:18 2008
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To: Ted Lemon <Ted.Lemon@nominum.com>
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: deprecating dangerous bit patterns and non-TC non-AXFR 
In-reply-to: Your message of "Thu, 21 Aug 2008 18:23:17 MST."
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> On Aug 21, 2008, at 5:56 PM, Masataka Ohta wrote:
> > Today, though TTL could be more than 1 second, which is already
> > quite unlikely,
> 
> I measured ping times to my home server at as much as 40 seconds  
> during the most recent IETF meeting.   Arguably, we could describe  
> this as an outage.  But unfortunately, there exist networks where  
> routers are configured with excessive buffering, or where the layer  
> two erroneously provides reliability.   On such networks, when there  
> is congestion, long round trip times are actually quite common.

	As are the inter arrival times for fragments.

> --
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-- 
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1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Thu Aug 21 19:38:05 2008
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Subject: Re: deprecating dangerous bit patterns and non-TC non-AXFR
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Mark Andrews wrote:

>>I measured ping times to my home server at as much as 40 seconds  
>>during the most recent IETF meeting.   Arguably, we could describe  
>>this as an outage.  But unfortunately, there exist networks where  
>>routers are configured with excessive buffering, or where the layer  
>>two erroneously provides reliability.   On such networks, when there  
>>is congestion, long round trip times are actually quite common.

> 	As are the inter arrival times for fragments.

That they are not even covered by the default reassembly timeout
means that we don't have to consider cases with wrongly large
buffers.

						Masataka Ohta


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From owner-namedroppers@ops.ietf.org  Thu Aug 21 20:22:24 2008
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Subject: Re: deprecating dangerous bit patterns and non-TC non-AXFR
Date: Thu, 21 Aug 2008 20:13:09 -0700
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On Aug 21, 2008, at 7:32 PM, Masataka Ohta wrote:
> That they are not even covered by the default reassembly timeout
> means that we don't have to consider cases with wrongly large
> buffers.

I think here we are speculating from nonexistent or anecdotal data.    
My general experience has been that where the network is basically  
working, but somewhat misconfigured, delays of up to 10 seconds are  
not uncommon.   The IETF network in Dublin is the first one I've been  
on where I've seen a response after 40 seconds.   I was quite  
astonished.


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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: SCTP (and DCCP) 
In-reply-to: Your message of "Fri, 22 Aug 2008 01:00:44 +0200."
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> Paul Vixie wrote:
> 
> > i see five reasons why SCTP is worth looking at as a primary transport with
> > UDP as its fallback.  first, data transfer can take place in the second
> > round trip (packets 3 and 4).  second, it has 32-bit ID fields so we could
> > go back to fixed port numbers perhaps even fixed+increment on TXID's.
> > third, we could mandate EDNS, and with it, we could mandate PING.  fourth,
> > SCTP has the idea of "passive" sockets which mean nonquadratic socket pool
> > sizes.  fifth, association timeout is handled in the stack not the app.
> 
> 
> All the things you talk about are engineering problems which are already 
> solved this day.
> 
> 
> It's no big issue these days to serve thousands of clients, be it TCP or 
> UDP. See [1] for common solutions to the problems, and [2] for 
> benchmarks in this area. Nowadays the amount of clients you can serve in 
> parallel are only limited by the amount of memory you've got for the 
> respective data structures and the performance of the operations which 
> are needed to traverse said data structures. RAM is cheap to come by, 
> and at least since fefe has pointed out outstanding issues in 
> implementations, every major OS should scale fine.

	The problem is not so much the server side.  It's the client
	side of the recursive nameserver.  You have to deal with
	running out of local ports especially when you need to lock
	down the source address.  Plain bind() + connect() won't
	scale.

	I suppose one could choose a single local source port then
	set SO_REUSEADDR before binding to the local address and
	port but then you can only have one socket in this state
	until you call connect.

	If you have multiple queries to the same server you have to
	do one or both of:
	* choose a new local port that is not being used to talk to
	  the remote server
	* or multiplex your queries down the one socket

> If your application isn't designed for such a task it takes a bit of 
> refactoring and a few hours back at the architecture board, but it is 
> feasible. Please do not try to design the protocols around your current 
> implementation but around current engineering standards.
> 
> 
> There's no need to go back to static source ports, the implementations 
> which are out there work quite fine. You could also mandate (or 
> "SHOULD", in RFC-speak) PING by now with the current UDP/TCP 
> infrastructure, it just needs a common vision and a common goal. If you 
> get the few major DNS vendors out there to support your cause, 
> everything should be fine (tm) in a few years worth (and much earlier 
> for those installations were people actually care about DNS).
> 
> 
> > i see two gigantic challenges for ANY non-UDP transport: installed base of
> > DNS protocol agents; installed base of firewalls and NATs and middleboxes.
> 
> Whereas changes in the TCP direction are much easier to come by than 
> SCTP/DCCP or any different "newfangled" protocol which installed base is 
> tremendeously exceeded by the amount of IPv6 production hosts ;).
> 
> Michael
> 
> [1] http://www.kegel.com/c10k.html
> [2] http://bulk.fefe.de/scalability/
> 
> --
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PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Fri Aug 22 00:05:19 2008
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Date: Fri, 22 Aug 2008 08:57:04 +0200
From: bert hubert <bert.hubert@netherlabs.nl>
To: Mark Andrews <Mark_Andrews@isc.org>
Cc: Michael Renner <robe@amd.co.at>, Paul Vixie <vixie@isc.org>,
	namedroppers@ops.ietf.org
Subject: Re: SCTP (and DCCP)
Message-ID: <20080822065704.GJ14116@outpost.ds9a.nl>
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On Fri, Aug 22, 2008 at 03:52:19PM +1000, Mark Andrews wrote:
> 	The problem is not so much the server side.  It's the client
> 	side of the recursive nameserver.  You have to deal with
> 	running out of local ports especially when you need to lock
> 	down the source address.  Plain bind() + connect() won't
> 	scale.

Fwiw, both dnscache (djbdns) and powerdns have been working with bound() and
connect()ed udp sockets for many years now.

So this problem does not appear to be an issue in the real world.

	Bert

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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        namedroppers@ops.ietf.org
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: SCTP (and DCCP) 
In-reply-to: Your message of "Fri, 22 Aug 2008 08:57:04 +0200."
             <20080822065704.GJ14116@outpost.ds9a.nl> 
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> On Fri, Aug 22, 2008 at 03:52:19PM +1000, Mark Andrews wrote:
> > 	The problem is not so much the server side.  It's the client
> > 	side of the recursive nameserver.  You have to deal with
> > 	running out of local ports especially when you need to lock
> > 	down the source address.  Plain bind() + connect() won't
> > 	scale.
> 
> Fwiw, both dnscache (djbdns) and powerdns have been working with bound() and
> connect()ed udp sockets for many years now.
> 
> So this problem does not appear to be an issue in the real world.
> 
> 	Bert

	I've been told unbound only has a maximum of 1000 active
	sockets and if you get more than that many outstanding
	recursive queries it stalls the new queries.

	I havn't looked at how djbdns deals with lots of simultanous
	queries.

	Mark
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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-----BEGIN PGP SIGNED MESSAGE-----
Hash: SHA1

Paul Vixie wrote:
> nominum, powerdns, and unbound are probably doing more than port
> randomization.  perhaps you can all three explain what you're doing, in
> detail, so that the WG can decide whether those are reasonable things to
> recommend to the rest of the community.

I am going to document the countermeasures I envision (in addition to
DNSSEC) for Unbound in a draft (as the wg chairs ask).

Best regards,
   Wouter
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From owner-namedroppers@ops.ietf.org  Fri Aug 22 09:17:25 2008
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> > nominum, powerdns, and unbound are probably doing more than port
> > randomization.  perhaps you can all three explain what you're doing, in
> > detail, so that the WG can decide whether those are reasonable things to
> > recommend to the rest of the community.
> 
> I am going to document the countermeasures I envision (in addition to
> DNSSEC) for Unbound in a draft (as the wg chairs ask).

that would be great.

it's my view that while implementors should of course innovate, there has to
be a documented standard, which is testable for both interoperability and
correctness, and which represents an adequate implementation level for what
we used to call "forgery resilience".  so while i'll be happy to see 
descriptions of what each implementor is doing, and i agree with ted lemon
that any form of "not wanting to discuss it in public" is counterproductive,
the end result has to be guidance to future implementors.  in that sense, we
know that randomizing the DNS-TXID and UDP-SRCPORT isn't good enough, and so
we have work to do.

beginning that work with a survey of methods now in practice would be good,
but the end result has to be a description of either a set of methods which
are considered adequate, or a set of attacks which a conformant
implementation must be able to resist, or both.

it's in that sense that i consider DNSSEC the final solution (since it
handles end-to-end attacks whether on- or off-path), and in which i would
consider PING, TCP, or SCTP partial solutions (since they only handle
off-path attacks).  whereas a laundry list of small things which implementors
could do and which some implementors are doing, is not a testable standard
for new implementors.


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Subject: Defending against the Kaminsky attack
Date: Fri, 22 Aug 2008 12:55:58 +0100
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[ Moderators note: Post was moderated, either because it was posted by
   a non-subscriber, or because it was over 20K.  
   With the massive amount of spam, it is easy to miss and therefore 
   delete relevant posts by non-subscribers. 
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I was wondering whether the Kaminsky attack can be defeated by methods othe=
r than adding more entropy.

I think it can. These thoughts are preliminary, came to me in my sleep last=
 night, so I may be mistaken.

o Attack
  Generate multiple questions
  type=3DA x1.bigbank.com
  type=3DA x2.bigbank.com
  type=3DA x3.bigbank.com
  ....
  Cache asks ns1.bigbank.com for each.=20
  Bailiwick is bigbank.com.
  Spoof response is:
  Question x1.bigbank.com
  Answers: Empty
  Authority: NS for bigbank.com is ns1.bigbank.com
  Additional: Host for ns1.bigbank.com is 10.0.0.99 ( IP address under cont=
rol of attacker )

  Is this suspicious?
  Yes. Authority record is not required, Bailiwick =3D LHS of authority rec=
ord.
  LHS of NS record should be properly within Bailiwick, this one isn't, it =
is equal.
  So record is invalid and should be discarded.

  Ok, what about this:
  Question x1.bigbank.com
  Answers: Empty
  Authority: NS for x1.bigbank.com is ns1.bigbank.com
  Additional: Host for ns1.bigbank.com is 10.0.0.99* ( attacker's IP addres=
s )

  Is this suspicious?
  Authority record is now ok.=20
  But glue record is not.=20
  Glue records should only be accepted if they LHS matches RHS of valid Aut=
hority record that needs glue.
  An authority record needs glue iff it is of form NS for xxxxx is somethin=
g.xxxxx

So, resolvers should make these checks.

Apologies in advance if this turns out to be nonsense, or is already well k=
nown.

I have not tested it, and am not sure if there are any implications for sta=
ndards.

George Barwood=

------=_NextPart_000_006B_01C90456.6C086D80
Content-Type: text/html;
 charset="iso-8859-1"
Content-Transfer-Encoding: quoted-printable

<!DOCTYPE HTML PUBLIC "-//W3C//DTD HTML 4.0 Transitional//EN">
<HTML><HEAD>
<META http-equiv=3DContent-Type content=3D"text/html; charset=3Diso-8859-1">
<META content=3D"MSHTML 6.00.6000.16705" name=3DGENERATOR>
<STYLE></STYLE>
</HEAD>
<BODY bgColor=3D#ffffff>
<DIV><FONT face=3DArial size=3D2>
<DIV><FONT face=3DArial size=3D2>I was wondering whether the Kaminsky attac=
k can be=20
defeated by methods other than adding more entropy.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>I think it can. These thoughts are prelimi=
nary,=20
came to me in my sleep last night, so I may be mistaken.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>o Attack<BR>&nbsp; Generate multiple=20
questions<BR>&nbsp; type=3DA x1.bigbank.com<BR>&nbsp; type=3DA=20
x2.bigbank.com<BR>&nbsp; type=3DA x3.bigbank.com<BR>&nbsp; ....<BR>&nbsp; C=
ache=20
asks ns1.bigbank.com for each. </FONT></DIV>
<DIV><FONT face=3DArial size=3D2>&nbsp; Bailiwick is bigbank.com.<BR>&nbsp;=
 Spoof=20
response is:<BR>&nbsp; Question x1.bigbank.com<BR>&nbsp; Answers:=20
Empty<BR>&nbsp; Authority: NS for bigbank.com is ns1.bigbank.com<BR>&nbsp;=
=20
Additional: Host for ns1.bigbank.com is 10.0.0.99 (&nbsp;IP address under=
=20
control of attacker )</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>&nbsp; Is this suspicious?<BR>&nbsp; Yes. =
Authority=20
record is not required, Bailiwick =3D LHS of authority record.<BR>&nbsp; LH=
S of NS=20
record should be properly within Bailiwick, this one isn't, it is=20
equal.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2>&nbsp; So record is invalid and should be=
=20
discarded.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>&nbsp; Ok, what about this:<BR>&nbsp; Ques=
tion=20
x1.bigbank.com<BR>&nbsp; Answers: Empty<BR>&nbsp; Authority: NS for=20
x1.bigbank.com is ns1.bigbank.com<BR>&nbsp; Additional: Host for ns1.bigban=
k.com=20
is 10.0.0.99* ( attacker's IP address )</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>&nbsp; Is this suspicious?<BR>&nbsp; Autho=
rity=20
record is now ok. <BR>&nbsp; But glue record is not. <BR>&nbsp; Glue record=
s=20
should only be accepted if they LHS matches RHS of valid Authority record t=
hat=20
needs glue.<BR>&nbsp; An authority record needs glue iff it is of form NS f=
or=20
xxxxx is something.xxxxx</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>So, resolvers should make these=20
checks.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>Apologies in advance if this turns out to =
be=20
nonsense, or is already well known.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>I have not tested it, and am not sure if t=
here are=20
any implications for standards.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>George=20
Barwood</FONT></DIV></FONT></DIV><br><br>
<P align=3Dcenter>&nbsp;&nbsp;</P>
</body></HTML>

------=_NextPart_000_006B_01C90456.6C086D80--



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From owner-namedroppers@ops.ietf.org  Fri Aug 22 09:30:54 2008
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Subject: Defining defense levels...
Date: Fri, 22 Aug 2008 09:25:37 -0700
Cc: Nicholas Weaver <nweaver@ICSI.Berkeley.EDU>
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One thought (again, I don't know how much this has been hashed out) is  
how robust do DNS resolvers REALLY need to be?

Any comments on the following?


I personally believe that resolvers should be robust to anything short  
of a man-in-the-middle ("Aware & Blocking"), yet man-in-the-middle is  
almost irrelevant for purposes of defending DNS.  [1]  Thus as long as  
the DNS resolvers are strong to anything short of the man-in-the- 
middle, its good in practice.

At the same time, such robustness must ONLY involve changes to the  
resolvers: the resolvers should be able to protect themselves, without  
relying on the authoritative servers making changes (although  
authoritative servers may suffer more load, especially servers which  
return some out-of-standard nonsenses.). [2]

And probabilistic protection is perfectly good.  We don't need perfect  
protection against blind attacks, we just need to ensure that the  
attacker resources involved are far better spent elsewhere.



My thoughts:

Against blind attacks, I believe the following principles should apply:

a)  No birthday attacks, of course.

b)  >=20b of entropy for purposes of protecting the transaction [3]

c)  >=40b of entropy for purposes of protecting the cache [4]

d)  Detecting when network entropy (port #) is reduced or eliminated  
by an in-path network device, allowing the resolver to accurately  
estimate the entropy it is generating in the requests.

e)  Detect and respond when there is .001% of a chance that a blind  
attack created one or more corrupt cache entries by either  
revalidating or voiding the cache.

f)  NO "race until win" scenarios for ANY given mapping in the cache.   
ALL blind attacks should be either "Race once per TTL" or "Race until  
another race until win".  Blind attacks should always cost time as  
well a packets.  [5]

ALL of the previous principles seem doable using existing techniques  
(port and 0x20 randomization, duplication, a single global counter to  
count unsolicited replies, and some seemingly simple data acceptance  
policies)



Against transparent attacks, I believe the following should apply:

If a resolver, within its normal transaction timeout, receives a  
second reply with a differing value but which would have been  
otherwise accepted (matching on TXID, port, server, 0x20, etc), this  
must be considered an attack on both the transaction and the cache. [6]

If the resolver is an intermediary, it MUST forward the second  
response back to the original requester, with the TTL for the "new"  
value set to 1 second.

For the resolver's cache, any entry which MAY have been potentially  
affected by the second reply MUST be treated as corrupted by an  
attack.  Thus, depending on how much information is recorded and  
available, various cache entries may need to be voided or undone (up  
to all cache entries for the domain in question, if more precise  
record keeping is unavailable).  Even if this would not be considered  
an attack, it doesn't actually make sense to cache anything which may  
have been dependent on this response.

For the final client, it is up to the client to determine what to do,  
but the strong suggestion is to consider this an attack and abort any  
transaction involving this name.

However, if the end client does not treat this as an attack and abort  
subsequent TCP connections to the final IP, this loss of transaction  
protection means that the few authorities which trigger this alert  
through "normal" behavior will simply see their results not cached  
rather than not accepted by the client.





[1] If an attacker can man-in-the-middle the naming stream of a  
victim, he can probably man-in-the-middle the data stream.  If the end  
protocol desired is weak to a man-in-the-middle, reliable naming does  
no good.  If the end protocol is robust to a man-in-the-middle, it  
never really trusted the DNS record.

[2] This is why I'm not a believer in DNSSEC.  It has both bad network  
effects (both the resolver and authority needs to change behavior, yet  
the changed behavior only protects the intersection of the two sets,  
so neither resolvers nor authorities have strong internal incentives  
to deploy), yet does not actually provide, to my mind, all that much  
meaningful system security because the other options available to a  
man-in-the-middle in practice.

[3] Blind transaction attacks, when combined with protections that  
provide "race once per TTL per name", as far as I can tell, only work  
against some seriously broken protocols.  By specifying a different  
level of protection for transactions and the cache, this allows  
duplication to protect the cache while still successfully resolving  
(but NOT caching) sites which return different values on back-to-back  
queries when duplication is needed to meet the entropy budget.

[4] Anyone who wants to launch a TB DOS to poison my cache has better  
things to do.

[5] I believe that the proper policy on accepting data into the cache  
can provide this, combined with treating a failure to lookup a name as  
an event with a ~30 second TTL.  This property is an important  
COMPLEMENT to increased entropy, not a substitute.  "Race until win"  
does not reduce the number of packets an attacker requires, only the  
time period.

[6] This will occur with high probability whenever there is a blind  
attack that doesn't also block the authoritative server or create  
traffic with a DOS condition.  It will ALSO occur with high  
probability if an attacker is able to directly observe the request to  
craft a reply, but is not fully in path.  More importantly, a  
preliminary survey survey suggests that only a few authorities  
actually do return such nonsense.


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From owner-namedroppers@ops.ietf.org  Fri Aug 22 11:19:44 2008
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Subject: Active countermeasures (threat or danger?)
Date: Fri, 22 Aug 2008 11:14:21 -0700
References: <200808211532.m7LFWJKx046469@givry.fdupont.fr> <40391.1219336326@nsa.vix.com> <20080821170545.GB14116@outpost.ds9a.nl> <49938.1219339836@nsa.vix.com>  <48AE9A88.5040707@nlnetlabs.nl>  <59927.1219421372@nsa.vix.com>
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On Aug 22, 2008, at 9:09 AM, Paul Vixie wrote:
>> I am going to document the countermeasures I envision (in addition to
>> DNSSEC) for Unbound in a draft (as the wg chairs ask).
>
> that would be great.

Dan raised the point on his blog recently that active countermeasures  
have the problem that they make a great avenue for denial-of-service  
attacks.   Seems like something worth keeping in mind.


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From owner-namedroppers@ops.ietf.org  Fri Aug 22 11:27:10 2008
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On Aug 22, 2008, at 9:25 AM, Nicholas Weaver wrote:
> And probabilistic protection is perfectly good.  We don't need perfect
> protection against blind attacks, we just need to ensure that the
> attacker resources involved are far better spent elsewhere.

This isn't strictly true, because there are on-path non-cache- 
poisoning attacks to DNS that are not MitM attacks but that let me  
reliably MitM your HTTP connections.   And these attacks are easily  
prevented with DNSSEC, and completely unpreventable with, e.g., port  
randomization.

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From owner-namedroppers@ops.ietf.org  Fri Aug 22 11:27:36 2008
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From:	 JINMEI Tatuya / =?ISO-2022-JP?B?GyRCP0BMQEMjOkgbKEI=?=
 <Jinmei_Tatuya@isc.org>
To:	 bert hubert <bert.hubert@netherlabs.nl>
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Subject: Re: how to spoof . by Kaminsky's method (Re: Agile countermeasures)
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At Thu, 21 Aug 2008 15:12:07 -0700,
JINMEI Tatuya <Jinmei_Tatuya@isc.org> wrote:

> > > - the recursive server replaces the forged NS RRset with the
> > >   legitimate one:
> > >   . IN NS [a-m].root-servers.net.
> > 
> > Well, you could do that - hardcode the list of root-servers. Is that what
> > people do?
> 
> Oops, I meant:
> 
> - the recursive server replaces the legitimate NS RRset for .
>   (which is normally) . IN NS [a-m].root-servers.net.
>   with the forged NS RRset
> 
> Is this what you had in your mind?

I've been hoping someone enlightens me, but there seems to be no luck.
So I'll continue speculating...

I've missed "answers" in the example given before:

: Send queries for '1.', '2.', '3.', '4.' etc to a resolver. In the meantime,
: blast it with answers for '1.', '2.' etc with new NS records of your choosing
: for '.'. Be sure to pick the source address of the nearest root-server.

so the intent is perhaps this one:

- the attacker (somehow) force the recursive server to send a query
  for (e.g.) '1. IN AAAA'
- then the attacker sends a forged response as follows:
  question: 1. IN AAAA
  answer 1. IN AAAA 2001:db8::1234
  authority: . IN NS evil.example.
  additional: evil.example. AAAA 2001:db8::1
- the recursive server replaces the legitimate NS RRset for .
  (which is normally) . IN NS [a-m].root-servers.net.
  with the forged NS RRset, possibly with the additional AAAA RRset

(Un)fortunately, this attack succeeds only in a very limited situation
as long as the recursive server performs "priming" (as described in
draft-koch-dnsop-resolver-priming-00) and follows the data ranking
concept described in Section 5.4.1 of RFC2181: the recursive server
should have a cached entry of "./NS" at the data rank of "The
authoritative data included in the answer section of an authoritative
reply" as a result of priming, while the rank of the forged authority
section is "Data from the authority section of an authoritative
answer".  So, the forged response cannot unconditionally replace the
existing cache.  This is one major difference for "."  from any other
domains.

The attacker could wait for the expiration of the high-rank cache;
however, the first query (which may or may not be caused by the
attacker) after the expiration will immediately trigger the next
priming and the high-rank data is soon cached again, so the possible
attackable window is very limited.  This is another major difference
for "." (+ the notion of priming) from any other names in the context
of Kaminsky's attack.

Of course, this defense depends on whether implementation diligently
performs priming and follows the data ranking rule of RFC2181.  One
implementation that I know very well behaves that way (I've actually
confirmed that by "attacking it" based on the above scenario); as far
as I can confirm, that's the only implementation that meets this
requirement, though.

In any event, this is probably a different attack scenario from what
you were thinking when you said this:

: 3) DNS-0x20 - although that doesn't protect the vital and scary . and COM
: records from numerical kaminsky attacks.

I'm very much interested in knowing that (if it's not secret:-).

---
JINMEI, Tatuya
Internet Systems Consortium, Inc.

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From owner-namedroppers@ops.ietf.org  Fri Aug 22 11:42:03 2008
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Subject: Re: Defining defense levels...
Date: Fri, 22 Aug 2008 11:37:06 -0700
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On Aug 22, 2008, at 11:23 AM, Ted Lemon wrote:
> On Aug 22, 2008, at 9:25 AM, Nicholas Weaver wrote:
>> And probabilistic protection is perfectly good.  We don't need  
>> perfect
>> protection against blind attacks, we just need to ensure that the
>> attacker resources involved are far better spent elsewhere.
>
> This isn't strictly true, because there are on-path non-cache- 
> poisoning attacks to DNS that are not MitM attacks but that let me  
> reliably MitM your HTTP connections.   And these attacks are easily  
> prevented with DNSSEC, and completely unpreventable with, e.g., port  
> randomization.

Those are "Aware" attackers, NOT blind attackers in the taxonomy I'm  
pushing, as they know the entropy of the request.

See http://www.ops.ietf.org/lists/namedroppers/namedroppers.2008/msg01459.html 
  for the taxonomy I'm using.


For such an attacker, the question is, are they "Transparent" or  
"Blocking": able to squelch the legitimate reply?

An Aware, Blocking attacker IS almost certainly a man in the middle  
(or a packet snoop who's also DOSing the authority with enough traffic  
that the requests fail, who you might as well call a MitM).

Such an attacker can just as easily directly MITM your TCP stream in  
almost all cases, because the path for the naming is almost certainly  
the path for the data.



An Aware, Transparent attacker (eg, a typical packet injector) you CAN  
detect by looking for mismatched responses: where you get two  
responses to the same query but with different values.  You can also  
MITIGATE such attack's damage to the cache, and NOTIFY the end client.

We used such a technique very successfully to detect injected TCP  
Reset packets, and if applied to DNS, the number of authoritative  
servers which return two responses to the same query but with  
different answers is VERY low.

And if the client is suitably paranoid, can treat as an attack in  
progress.

The probability of detecting being just the probability that the  
legitimate response is returned by the authoritative server.


This is why I try to be precise about taxonomy.

Or is there some form of attacker who's not blind but doesn't know the  
entropy of the request?



What holes are there in the following two axes of taxonomy:

Blind vs Aware:  Does the attacker have to guess or does he know the  
entropy of the request?

Transparent vs Blocking: Is the legitimate response processed and  
returned by the legitimate authority, or is the attacker able to block  
the legitimate request processing?


And which attackers are "Aware" (see the packets, assuming a good  
server), "Blocking" (able to block the request) other than either a  
full man-in-the-middle on your DNS flows or someone snooping packets  
on your DNS flows who's also creating/taking advantage of a DOS  
situation?


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On Aug 22, 2008, at 11:14 AM, Ted Lemon wrote:

> On Aug 22, 2008, at 9:09 AM, Paul Vixie wrote:
>>> I am going to document the countermeasures I envision (in addition  
>>> to
>>> DNSSEC) for Unbound in a draft (as the wg chairs ask).
>>
>> that would be great.
>
> Dan raised the point on his blog recently that active  
> countermeasures have the problem that they make a great avenue for  
> denial-of-service attacks.   Seems like something worth keeping in  
> mind.

You can and should bound these.  EG, if your active countermeasure is  
draconian (flush or revalidate the cache) when the attacker has a . 
001% chance of putting in one or more bad entries in a blind manner,  
by maintaning a simple count:

For 32b entropy for cached transactions, it doesn't work.  With a  
relatively small number of packets (less than 10,000), you'd cause a  
cache flush/revalidate.  Owch.

For 40b entropy for cached transactions, it can work fine.  Now the  
attacker needs 10M packets.  If your cache has only 1M entries active  
that you reload, this hardly seems economical as a DOS attack.


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On Aug 22, 2008, at 11:37 AM, Nicholas Weaver wrote:
> An Aware, Transparent attacker (eg, a typical packet injector) you CAN
> detect by looking for mismatched responses: where you get two
> responses to the same query but with different values.  You can also
> MITIGATE such attack's damage to the cache, and NOTIFY the end client.

This only works if the attacker follows the rules.   If the attacker  
jams the 802.11g network during the time when the response is  
expected, you'll see a short stutter in the network, and probably not  
notice it.   And since the jamming happened at the link layer, it will  
just look to the resolver like no packets arrived except the  
attacker's packets.

I suspect that producing a jammer that could be finely controlled in  
this way would be about a day's work for a knowledgeable  
practitioner.   My point being that this is not at all an expensive  
attack.   It's something I could do on the IETF meeting network and  
probably completely escape notice.


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Date: Fri, 22 Aug 2008 12:08:27 -0700
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On Aug 22, 2008, at 11:53 AM, Ted Lemon wrote:

> On Aug 22, 2008, at 11:37 AM, Nicholas Weaver wrote:
>> An Aware, Transparent attacker (eg, a typical packet injector) you  
>> CAN
>> detect by looking for mismatched responses: where you get two
>> responses to the same query but with different values.  You can also
>> MITIGATE such attack's damage to the cache, and NOTIFY the end  
>> client.
>
> This only works if the attacker follows the rules.   If the attacker  
> jams the 802.11g network during the time when the response is  
> expected, you'll see a short stutter in the network, and probably  
> not notice it.   And since the jamming happened at the link layer,  
> it will just look to the resolver like no packets arrived except the  
> attacker's packets.
>
> I suspect that producing a jammer that could be finely controlled in  
> this way would be about a day's work for a knowledgeable  
> practitioner.   My point being that this is not at all an expensive  
> attack.   It's something I could do on the IETF meeting network and  
> probably completely escape notice.
>

However, such a jammer can JUST AS EASILY be a MITM on the TCP stream  
itself!

Thats my point.


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On Aug 22, 2008, at 12:08 PM, Nicholas Weaver wrote:
> However, such a jammer can JUST AS EASILY be a MITM on the TCP stream
> itself!

No, in order to do this you'd have to jam continuously, which would be  
noticed.


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On Aug 22, 2008, at 12:14 PM, Ted Lemon wrote:

> On Aug 22, 2008, at 12:08 PM, Nicholas Weaver wrote:
>> However, such a jammer can JUST AS EASILY be a MITM on the TCP stream
>> itself!
>
> No, in order to do this you'd have to jam continuously, which would  
> be noticed.
>

Not really.

A:  End hosts don't notice currently: airpwn and Cookie Monster work  
just fine today.  Write your own in Click, its easy!

B:  With the low latency of the local LAN vs remote behavior, I can  
launch the nice airpwning completely by the time the legit SYN gets  
back.

C:  I could just ARP cache poison you and MITM that way...

D:  I could DHCP poison you when you first connect and MITM that way...

etc etc etc.

Against an adversary on the local wireless network, you have to assume  
either full end-to-end crypto on the final application or you are  
sunk.  Period

In such a threat model, DNSSEC buys almost nothing.


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On Aug 22, 2008, at 12:20 PM, Nicholas Weaver wrote:
> Against an adversary on the local wireless network, you have to assume
> either full end-to-end crypto on the final application or you are
> sunk.  Period

Opportunites to jam DHCP are infrequent.  Jamming an entire TCP stream  
is hard, and you only have to miss once to get caught.   Jamming  
single DNS transactions is easy, and opportunities to do will be  
frequent.  If you miss, you don't get caught - the traffic just goes  
through.

What's nice about DNSSEC is that there's no user in the loop.   To jam  
DNSSEC, you have to actually break the protocol - you can't just  
convince the user not to use it.   It's true that SSL will protect you  
if you use it correctly, but whether or not you use correctly it  
depends on the user.

I think you're seriously discounting the importance of human factors  
when you say that the security of the DNS channel doesn't matter.


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those are pattern-specific poison avoidances.  i'd much rather we focus
on not accepting the bad response than on not letting its content hurt us.

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At Fri, 22 Aug 2008 12:40:34 -0700,
Ted Lemon wrote:
At Fri, 22 Aug 2008 12:40:34 -0700,
Ted Lemon wrote:
> 
> On Aug 22, 2008, at 12:20 PM, Nicholas Weaver wrote:
> > Against an adversary on the local wireless network, you have to assume
> > either full end-to-end crypto on the final application or you are
> > sunk.  Period
> 
> Opportunites to jam DHCP are infrequent.  Jamming an entire TCP stream  
> is hard, and you only have to miss once to get caught.   Jamming  
> single DNS transactions is easy, and opportunities to do will be  
> frequent.  If you miss, you don't get caught - the traffic just goes  
> through.
> 
> What's nice about DNSSEC is that there's no user in the loop.   To jam  
> DNSSEC, you have to actually break the protocol - you can't just  
> convince the user not to use it.   It's true that SSL will protect you  
> if you use it correctly, but whether or not you use correctly it  
> depends on the user.
> 
> I think you're seriously discounting the importance of human factors  
> when you say that the security of the DNS channel doesn't matter.

Without getting into some sort of huge SSL vs. DNSSEC debate, I'd 
be interested in hearing what you think "using it correctly" 
consists of. 

Do you mean that the SSL implementations allow the user to override
things that look like security errors to the stack. If so, the stack
could, of course, refuse to let you do anything it thought was unsafe
(indeed, some older browsers did this) but experience indicates that
users find this intolerable. If your argument is that DNSSEC is better
because you don't get an opportunity to override the stack, I think
there's some room for debate about whether that's really an improvement.

-Ekr





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On Aug 22, 2008, at 12:40 PM, Ted Lemon wrote:

> On Aug 22, 2008, at 12:20 PM, Nicholas Weaver wrote:
>> Against an adversary on the local wireless network, you have to  
>> assume
>> either full end-to-end crypto on the final application or you are
>> sunk.  Period
>
> Opportunites to jam DHCP are infrequent.  Jamming an entire TCP  
> stream is hard, and you only have to miss once to get caught.    
> Jamming single DNS transactions is easy, and opportunities to do  
> will be frequent.  If you miss, you don't get caught - the traffic  
> just goes through.

Actually, its easy.  You force the user to dissassociate and  
reassociate, there are attacks for that.  Voila.  Access point, DHCP,  
ARP, take your pick.  You can spoof em all.

And for most TCP attacks, you don't actually need to jam because the  
recipients aren't looking for mismatches.  Spoof the SYN/ACK, chat  
away, and be happy.  It works like a charm!  Every time.

As a bonus, since apart from the real SYN/ACK (which you CAN jam using  
your method), most remote systems won't actually send RST packets to  
these "unsolicited" data packets it sees, and even if they do, as long  
as you keep the data flowing, any RST will be out of sequence and  
ignored on the recipient.

So you CAN actually MITM TCP, WITH a jamming property, against most  
systems in practice on the wireless network, because most won't send  
the RSTs that the packets say in the first place these days, so all  
you need to jam is the SYN/ACK

> What's nice about DNSSEC is that there's no user in the loop.   To  
> jam DNSSEC, you have to actually break the protocol - you can't just  
> convince the user not to use it.   It's true that SSL will protect  
> you if you use it correctly, but whether or not you use correctly it  
> depends on the user.


But, see the above, even with the fully secured NAME->IP mapping, you  
are still in the exact same position in your attack scenario:  
completely h0zed unless the user's actual protocol supports end-to-end  
crypto right.



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On Aug 22, 2008, at 1:33 PM, Nicholas Weaver wrote:
> But, see the above, even with the fully secured NAME->IP mapping, you
> are still in the exact same position in your attack scenario:
> completely h0zed unless the user's actual protocol supports end-to-end
> crypto right.

On reflection, I think that I am arguing about the wrong thing.    
You're right that DNSSEC doesn't stop a MitM attack.   A smart  
attacker would allow DNS to flow freely, and attack elsewhere, if they  
controlled your link to the rest of the world.   To protect against  
this would require much more careful use of SSL than is common at  
present, and DNSSEC would not help.

However, there's a case that you haven't really covered in your  
analysis.   That's the case where the attacker gains control of the  
local cache.   They don't have control of the path, but because they  
control the cache, they can convince you to send packets to them  
instead of to the correct destination.   Your detection heuristics  
would completely fail here, because there's no competition between a  
blind or transparent attacker and the cache - the attacker *is* the  
cache.

Also, you propose is that we just assume the answer we receive is  
correct, and abort the transaction if it turns out not to be.   But  
the security handshake is probably finished at this point, and the  
private data has been leaked to the attacker.   And we don't *know*  
that the data has leaked - we just think it has.   So we're  
potentially going to be exposing the user to false positives that will  
train them to click through whatever warnings we might present.

You could kludge around this a bit by choosing a wait time shorter  
than the maximum timeout, and not starting the transaction before  
that.   But to get any degree of reliability, I think you'd have to  
introduce unacceptable delays.

Also, you assume that the application designers will get it right.    
My app has to have a way of receiving an out-of-band notification from  
the resolver to tell me to abort the transaction, and I have to abort  
the transaction in a way that is appropriate to the circumstances, up  
to and including telling the user they need to change their password  
pronto.

In the case of a web app, the engine that would have to make this  
decision (the browser) doesn't really even know the security model of  
the web app, so it's really not going to be able to give appropriate  
advice to the user.   This window of opportunity introduces a degree  
of complexity to trusted apps that I think is unlikely to work in  
practice, even if it could work in theory.

By contrast, if we validate the DNS response before we use it, we  
close off these windows of opportunity completely.   We certainly do  
not eliminate all avenues of attack, but we do eliminate this one.


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From owner-namedroppers@ops.ietf.org  Sat Aug 23 01:42:25 2008
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From: bert hubert <bert.hubert@netherlabs.nl>
To: Paul Vixie <vixie@isc.org>
Cc: namedroppers@ops.ietf.org
Subject: Re: Agile countermeasures
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On Thu, Aug 21, 2008 at 10:12:46PM +0200, bert hubert wrote:
> A more advanced way is:
> 
> 5) Stop accepting new data below the attacked apex, but also stop expiring
> it.

Ok, I've been pondering another one, and I wonder if it will work. 

While under attack, 

5a) become ultra-paranoid and don't accept any data except the first answer
    record. Ignore new NS records, CNAME chains, additional records etc.

    This would make the NSSet of the attacked domain expire, but it would be
    refreshed from the parent zone when that happens.

    While the attacker could try to target that event as well, it too would
    be detected.

An attacker can then still take over xaaaaaaaaa.ietf.org, but he won't be
able to spread this to the NS records.

	Bert

-- 
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> ...
> While under attack, 
> ...

for the sake of future implementors whom this WG must guide via documents
produced in this early part of the kaminsky era, i am still hoping for a
non-modal solution.  this is because conformance and interoperability
testing of protocol implementations is already quite hard, and if we have
to test "does it go into the attack mode under the right conditions" as
well as "can it in that mode resist the attacks we know of" then it makes
a test cost multiplicative that could otherwise have been additive.

thus PING, 0x20, DNSSEC, SCTP loom larger for me than detecting attacks
and behaving differently during attacks.  nick weaver and masataka ohta
have each made some non-modal proposals about noncaching of data, and i
think the WG should seriously investigate, and prefer, non-modal proposals.
if in the end we can't find a solution that doesn't involve adding IDS to
DNS, then so be it.  but the main thrust of our effort should be non-modal.

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From: bert hubert <bert.hubert@netherlabs.nl>
To: Paul Vixie <vixie@isc.org>
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Subject: Re: Agile countermeasures
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On Sat, Aug 23, 2008 at 03:18:04PM +0000, Paul Vixie wrote:

> think the WG should seriously investigate, and prefer, non-modal proposals.
> if in the end we can't find a solution that doesn't involve adding IDS to
> DNS, then so be it.  but the main thrust of our effort should be non-modal.

If we can find such a solution, it would be wonderful. 

I've been working on a paranoid rrset acceptance mode today, perhaps it will
prove possible to fine-tune it such that it won't hurt (too much) and can be
left on all the time.

At the expense of some extra queries perhaps.

	Bert

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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From owner-namedroppers@ops.ietf.org  Sat Aug 23 08:39:11 2008
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> > ... the WG should seriously investigate, and prefer, non-modal proposals.
> > if in the end we can't find a solution that doesn't involve adding IDS to
> > DNS, then so be it.  but the main thrust of our effort should be non-modal.
> 
> If we can find such a solution, it would be wonderful. 

are we *all* agreed on this, then?

> I've been working on a paranoid rrset acceptance mode today, perhaps it will
> prove possible to fine-tune it such that it won't hurt (too much) and can be
> left on all the time.
> 
> At the expense of some extra queries perhaps.

that's the area nick weaver's also working in.  for many values of "some" that
don't involve "too much" new state (storage or maintainance) this sounds good
to me.

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From owner-namedroppers@ops.ietf.org  Sun Aug 24 07:25:22 2008
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From: Francis Dupont <Francis.Dupont@fdupont.fr>
To: Paul Vixie <vixie@isc.org>
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Subject: Re: SCTP (and DCCP) 
In-reply-to: Your message of Thu, 21 Aug 2008 16:32:06 -0000.
             <40391.1219336326@nsa.vix.com> 
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 In your previous mail you wrote:

   here are two articles on dnsop by bill fumerola in response to this thread
   there.

=> this shows the fall of T/TCP has left a hole...

   since sctp is slightly older and is used in ip telephony and is
   implemented on more systems and allows data transfer on the second round
   trip (packets 3 and 4), i'm more hopeful for it than i am for DCCP.
   
=> what we want is data transfer on the first round (packets 1 and 2)
but it opens the door to fake source (in packet 1) attacks...
DCCP is younger but its "market" is far larger. My concern is no
new transport can really replace UDP and as a DNS fallback TCP.

   i see five reasons why SCTP is worth looking at as a primary transport with
   UDP as its fallback.  first, data transfer can take place in the second
   round trip (packets 3 and 4).  second, it has 32-bit ID fields so we could
   go back to fixed port numbers perhaps even fixed+increment on TXID's.
   third, we could mandate EDNS, and with it, we could mandate PING.  fourth,
   SCTP has the idea of "passive" sockets which mean nonquadratic socket pool
   sizes.  fifth, association timeout is handled in the stack not the app.
   
=> IMHO this only shows SCTP has the pros and cons of a new transport.

Thanks

Francis.Dupont@fdupont.fr

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From owner-namedroppers@ops.ietf.org  Sun Aug 24 08:47:28 2008
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>    since sctp is slightly older and is used in ip telephony and is
>    implemented on more systems and allows data transfer on the second round
>    trip (packets 3 and 4), i'm more hopeful for it than i am for DCCP.
>    
> => what we want is data transfer on the first round (packets 1 and 2)
> but it opens the door to fake source (in packet 1) attacks...

yes, but to get data transfer in the first round trip, requires DNSSEC or
PING.  so i'm considering the impact of leaving SCTP associations open for
some period of time (there's an automatic association timeout handled in
the stack rather than in the application).  this would allow a "working set"
of associations who had already been through their first round trip.  it's
important to distinguish this from the TCP case where each session requires
its own socket descriptor on every stack now known to exist, thus placing a
giant burden on the application to do session management.  an SCTP app could
have tens or hundreds of thousands of associations open on a single "socket".

i see that neither DCCP nor SCTP transfers user data in its first round trip.
both offer message semantics (like UDP does), so the receiver can know the
size of the message without having to encode it into the stream as we do in
TCP/53.  DCCP relies on ip fragmentation to send messages larger than PMTU,
whereas SCTP is like TCP in that it can segment messages into IP packets that
are not larger than PMTU.  DCCP has no concept of "associations" like SCTP's
and cannot multiplex many pseudosessions across a single "socket" or whatever
the local stack calls its network endpoints.

> DCCP is younger but its "market" is far larger.

by "larger" do you mean "number of flows now using it" or something else?
the wikipedia pages for DCCP and SCTP show many more implementations of
SCTP.  

> My concern is no new transport can really replace UDP and as a DNS
> fallback TCP.

this is my concern also.  however, speaking from the point of view of RFC
2671, ip fragmentation is a disaster and anything that depends on it will
be very difficult to deploy.  if the DNS engineering community seriously
believes that DNS messages larger than PMTU must become commonplace some
day, then we have millions of firewalls and middleboxes and even routers
and switches to upgrade or replace.  

the truth of <http://www.ietf.org/proceedings/06jul/slides/tsvarea-1.pdf>
had not dawned on me at the time RFC 2671 was being prepared, though it's
all blazingly clearly true after N years of trying to get RFC 2671 deployed.
it's my opinion that the title of the RFC that resulted from this (RFC 4963)
does not do justice to the content.  ipv6 fragmentation doesn't have these
problems, so perhaps if we look to the future we can forget how terrible
ipv4 fragmentation really is.

>    i see five reasons why SCTP is worth looking at as a primary transport
>    with UDP as its fallback.  first, ....  second, ....  third, ....
>    fourth, SCTP has the idea of "passive" sockets which mean nonquadratic
>    socket pool sizes.  fifth, association timeout is handled in the stack
>    not the app.
>    
> => IMHO this only shows SCTP has the pros and cons of a new transport.

compared to UDP, TCP, or DCCP, reasons four and five (left intact above) are
unique to SCTP.  but the fundamental premise that it's likely impossible to
insert a new primary transport ahead of UDP/53 is one we all agree with.  if
i could be sure there would be reliable and instantanenous signalling of the
absence or failure of a new transport, and that we would not have to wait
for some kind of timeout to tell us that it wasn't going to work, i'd say we
should opportunistically deploy.  alas, RFC 2671 deployment experience shows
that a vast number of failures are inferrable only by timeouts.  middleboxes
(NATs, ALGs, firewalls) are exactly the bane the end-to-end crowd said they'd
be, and now we're hamstrung.

HTTP/1.1 with an XML schema for DNS messages would be more likely to succeed,
especially if we used TCP/80 and a RESTful API.  the internet isn't the web,
but enough endpoints are confused about the differences that deployability is
now generally higher for new web apps than it is for new internet apps.  sad.


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From owner-namedroppers@ops.ietf.org  Sun Aug 24 16:03:20 2008
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Paul Vixie wrote:
>
>   nick weaver and masataka ohta
> have each made some non-modal proposals about noncaching of data, and i
> think the WG should seriously investigate, and prefer, non-modal proposals.

I've been giving some thought to some of the underlying vulnerabilities, 
where the following intersect:
- the protocols involved
- the strategies of resolvers
- the data in the root and TLD *zones* (emphasis on zone vs domain)

At the root of the Kaminsky vulnerability is the ability to feed data 
into a cache, where the data in question
is provided in the "Additional" section.

If we ignore, for the moment, when/whether/what referrals are provided 
by servers in "Authority" sections,
and consider only the case of "if there *is* an authority section", then:

The Question:
When is it strictly necessary that Additional section data be provided 
*and* used (cached)?


(Undoubtedly there are cases where it is absolutely necessary, to bridge 
the gap at a zone cut.
If you have "example.com    NS    ns1.example.com", the only possible 
way for an empty cache to resolve the address of ns1.example.com, is via 
glue A/AAAA RR's.)

But first, a quick sidebar...


Sidebar: namespace congruity and phantom namespace

The main axiom of "the Domain Name System", is the "the".  (At least, 
for the public DNS sanctioned by ICANN et al.) There is only one.
The name space is hierarchical, and delegations occur at zone cuts.
Any legitimate, actual leaf in the name space must be reachable by 
starting at the root, and possibly crossing one or more zone cuts, 
reaching a terminal node in the label space of some leaf zone.

Depending on the domain names of NS RR's used in delegations (at zone 
cuts), with attendant glue A/AAAA records, it may be possible to 
establish "phantom leaf" labels in the name space which are not 
reachable via top-down tree walking, because one or more parent domains 
of the NS RR's do not exist.

If there were, for example, "example.com     NS    example.bar" with 
"example.bar    A    10.1.2.3", if the caching resolver accepted that 
delegation, a new, non-existent TLD, "bar." with one leaf entry, 
"example.bar", would suddenly exist in the resolver's cache.

Obviously, this is not something intentional, nor is it something that 
should generally be considered acceptable practice.

(end of sidebar)

If we exclude, axiomatically, the legitimacy of such "phantom" namespace 
elements, then we can then say the following are true:
- every leaf entry in the public DNS exists (and is served 
authoritatively) in one zone only
- every legitimate zone is delegated from its parent zone at a zone cut 
boundary
- every legitimate zone is served by one or more name servers, who serve 
that zone authoritatively
- every legitimate zone is anchored directly or indirectly at the root 
"." of the public DNS

Taking the above together, then, it would be sufficient for resolving 
anything legitimate in the public DNS, for glue A/AAAA RR's to exist 
only in the immediate parent's zone.
(I can elaborate on this if anyone wants, but I'm trying to keep this 
short).

Thus, The Answer:
If the *actual* glue A/AAAA RR's in (at a minimum) the root and all TLD 
zones met this condition, then the only time a resolver would ever 
*need* to accept "Additional" data would be in those exact cases, where 
the "Additional" data were given in the answer to a query for an A/AAAA 
RR, where the "Question" was for the RHS of a delegation, which was 
subordinate to (i.e. a child of) the LHS of the delegation.

What this means:
That the "Additional" section could be ignored in all other cases.

And I *think* this would, in turn, result in the "birthday attack" race 
only being run when the TTL of glue A/AAAA RR's expires.

Note also, that there will generally be orders of magnitude more NS 
entries pointing to the same RHS, and thus many fewer such races being 
run generally.

As a data point, I examined a pretty big TLD (org), and verified that no 
out-of-zone glue A/AAAA RR's exist - only subordinate A/AAAA glue RR's 
exist.
(If other TLD operators wouldn't mind checking this, and providing 
similar data points, I think we could possibly consider standardizing 
the non-use of Additional data.)

Brian Dickson

P.S. There is an important Corollary to the above:
There is nothing in the naming of nameservers (in NS records) that 
restricts the levels of indirection that can occur, between the names of 
zones served, and the names of the nameservers serving those zones.
As a practical matter, operators of nameservers *SHOULD* make reasonable 
efforts to limit the actual levels of indirection.
And, ideally, nameservers *should*, if possible and practical, be 
authoritative for their own names. If I have ns1.foo.example.com, and 
ask it for the A RR for ns1.foo.example.com, life is easier if it gives 
the answer, and does so authoritatively, *and* is itself listed in the 
NS RR set for the domain foo.example.com.

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From owner-namedroppers@ops.ietf.org  Sun Aug 24 19:21:43 2008
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> From: Brian Dickson <briand@ca.afilias.info>
> To: Paul Vixie <vixie@isc.org>
> CC: bert hubert <bert.hubert@netherlabs.nl>, namedroppers@ops.ietf.org, 
>  dns-operations@lists.oarci.net

plz don't ever crosspost between namedroppers and dnsops.  no possible
article is of interest to both audiences.  i'm removing dnsops, as well
as bert and brian since i know they are on namedroppers.

> ...
> At the root of the Kaminsky vulnerability is the ability to feed data
> into a cache, where the data in question is provided in the "Additional"
> section.

no.  the root of the kaminsky vulnerability is the ability to run a race
more than once and with a head start.  actual pollution can come in the
answer section (cname chains passing through or ending in names one wishes
to pollute), the authority section (replacement NS RRs for the baliwick
apex, or new subdomains of the baliwick), or the additional section (after
kashpureff resistance has been applied there are still many forms of evil
given the ability to arbitrarily populate the answer and authority sections.)

it's a mistake to focus on any one section or any one form of pollution.
the reason i'm enamored (in general, though there are many problems left
to solve in the proposals) of the approaches advocated by masataka ohta
and nick weaver is that they start from the question, what of all this do
we HAVE to believe, and why, and what's the cost of disbelief, and what
are our alternative means of acquiring the data, and what are the costs of
those alternatives, and furthermore, what does "belief" really mean?  in
other words, how can we "fail closed".

note that there may be other ways to achieve the "kaminsky effect" that do
not involve misdirection.  if an RDNS fails to implement birthday protection
(sends multiple simultaneous upstream queries for a given q-tuple), or fails
to cache the result (an rrset, or an nxdomain, or a nodata condition) for a
given q-tuple, or if an ADNS deterministically never answers some kinds of
questions (like undefined qtypes), or if a middlebox deterministically drops
some kinds of questions or some kinds of answers (like qtypes unknown to it)
then the "kaminsky effect" might be produced without the "sibling name trick"
and in those cases the answer matching the q-type could also be poisonous.

so even while my own toy RDNS now refuses to replace NS RRsets, and does not
cache any answer RRsets other than the one matching the q-tuple, and fully
implements RFC 2181's rrset credibility logic, and fully implements dns-0x20,
i do not feel "safe" yet.  when i can successfully reason from the starting
point "what should i use or keep?" rather than "what shouldn't i use or keep?"
then i'll be on a path that could lead to feeling safe.

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From owner-namedroppers@ops.ietf.org  Mon Aug 25 04:46:57 2008
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* Paul Vixie:

>> > ... the WG should seriously investigate, and prefer, non-modal proposa=
ls.
>> > if in the end we can't find a solution that doesn't involve adding IDS=
 to
>> > DNS, then so be it.  but the main thrust of our effort should be non-m=
odal.
>>=20
>> If we can find such a solution, it would be wonderful.=20
>
> are we *all* agreed on this, then?

I'm not sure---"does not support 0x20" or "does not support PING" as
an additional upstream attribute is kind of modal, too.

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=DFe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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From owner-namedroppers@ops.ietf.org  Mon Aug 25 04:48:53 2008
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From: "W.C.A. Wijngaards" <wouter@nlnetlabs.nl>
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Hi,

I've submitted a draft with the resolver side mitigations that I
envision for Unbound.

http://www.ietf.org/internet-drafts/draft-wijngaards-dnsext-resolver-side-mitigation-00.txt

Best regards,
   Wouter

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From owner-namedroppers@ops.ietf.org  Mon Aug 25 05:55:11 2008
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To: Ted Lemon <Ted.Lemon@nominum.com>
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Subject: Re: Defining defense levels...
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Ted Lemon wrote:

> What's nice about DNSSEC is that there's no user in the loop.   To jam  
> DNSSEC, you have to actually break the protocol

No. It is enough to break a zone in the loop.

> It's true that SSL will protect you  
> if you use it correctly, but whether or not you use correctly it  
> depends on the user.

Security of SSL, DNS or PKI in general depends both on the user and
intermediate administrators.

> I think you're seriously discounting the importance of human factors  
> when you say that the security of the DNS channel doesn't matter.

You're seriously discounting the importance of human factors  
when you say that the security of the DNS channels through zones
don't matter.

PKI, including but not limited to DNSSEC, is merely weakly secure
and is subject to MitM attacks.

						Masataka Ohta




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Date: Mon, 25 Aug 2008 22:47:37 +0900
From: Masataka Ohta <mohta@necom830.hpcl.titech.ac.jp>
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CC: Brian Dickson <briand@ca.afilias.info>, Paul Vixie <vixie@isc.org>, 
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Mark Andrews wrote:

> 	I can create delegations that REQUIRE glue from "DE" for
> 	zones under "COM" and glue in "COM" for zones under "DE"
> 	for the delegations to work.
> 
> 	e.g.
> 		example.de	NS ns1.example.com
> 		example.com	NS ns1.example.de
> 
> 	Back about BIND 4.9.[23] I configured named to stop accepting
> 	glue that wasn't under the parent zone.  I did this so I
> 	could chase down bad glue.  If there was bad glue I knew
> 	it had to come for a parent, grandparent etc.  I also knew
> 	that it would break delegations like the one I'm describing
> 	above but I also knew they were rare.

And your false assertions have resulted in BIND vulnerabilities
against Kaminsky's variation of ID guessing attacks.

Isn't it enough that both "bailiwick" and "PKI" are not secure,
not even theoretically.

						Masataka Ohta


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Subject: Re: Defining defense levels...
Date: Mon, 25 Aug 2008 08:55:26 -0700
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On Aug 25, 2008, at 5:48 AM, Masataka Ohta wrote:
>> I think you're seriously discounting the importance of human factors
>> when you say that the security of the DNS channel doesn't matter.
>
> You're seriously discounting the importance of human factors
> when you say that the security of the DNS channels through zones
> don't matter.

Ohta-san, the way argument works is that you make a statement, and  
then you give a reason why it's true.   And then if I agree with your  
reason, and agree that your reason applies, I have to agree with your  
statement.   Just making a statement isn't enough - if we do that,  
then we wind up just contradicting each other over and over, and never  
coming to a conclusion.

The problem with your thinking here is that it's _always_ true that if  
the server for a zone is pwned, you can't trust the contents of the  
zone or subzone of that zone, because the person who pwned the server  
can arbitrarily modify the data the server serves.

With DNSSEC, however, there are two differences.   First of all, if  
the server has not been pwned, then bogus data inserted by a third  
party will be detected.   This is because the zone has been signed,  
and there exists a validation path that can be used to verify that  
signature.

The second difference is that with DNSSEC, the mere fact that the  
server has been pwned does not *necessarily* mean that the signing key  
has been revealed.   This is because the administrator has a choice as  
to where to do zone signing - it need not be done on the same machine  
that serves the zone.   So in the case of DNSSEC, a sufficiently  
paranoid security policy protects against a vulnerability that PODS  
simply cannot protect against.

There are still ways to forge the contents of a DNS zone.   But they  
all involve getting access to the signing key for that zone.   So yes,  
DNSSEC is not a panacea.   If you ever thought that I was arguing that  
it is, please stop trying to convince me of that - I already realize  
that that is the case.


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From owner-namedroppers@ops.ietf.org  Mon Aug 25 12:03:07 2008
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Subject: Publication request for
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Mark,

This is a request to publish the document as Standards Track document,

Title           : Measures for making DNS more resilient against forged answers
Author(s)       : A. Hubert, R. van Mook
Filename        : draft-ietf-dnsext-forgery-resilience-07.txt
Date            : August 25 2008
Document shepherd: Olafur Gudmundsson ogud@ogud.com


1) Have the chairs personally reviewed this version of the ID and do
     they believe this ID is sufficiently baked to forward to the IESG
     for publication?

There is one nit according to idnits 2.08.10 (via tools.ietf.org).
The nit is that Informational RFC 3833 is a normative reference.
RFC 3833 is about the DNS threat model, this document addresses one of the
treats identified in RFC 3833 and describes techniques to make it harder
to exploit that particular threat.
We are not sure the reference should be moved between sections or not.


2) Has the document had adequate review from both key WG members and
     key non-WG members? Do you have any concerns about the depth or
     breadth of the reviews that have been performed?


Yes during last-call this document has been reviewed in depth by
a large number of working group members.
This particular document and the recent DNS exploits that attempt to
poison DNS caches, have brought number of new people to the working group.
We have no issue with the extent of reviews.

There is strong consensus to advance the document.

3) Do you have concerns that the document needs more review from a
     particular (broader) perspective (e.g., security, operational
     complexity, someone familiar with AAA, etc.)?

We think this document has had sufficient review.

4) Do you have any specific concerns/issues with this document that
     you believe the ADs and/or IESG should be aware of? For example,
     perhaps you are uncomfortable with certain parts of the document,
     or whether there really is a need for it, etc., but at the same
     time these issues have been discussed in the WG and the WG has
     indicated it wishes to advance the document anyway.


The only issues that people brought up are:
         Standards track vs. BCP.
         The TCP fallback

On the first one most people stated preference to one or the other but at
the same time said they could live with the other.
The requirement in section 9 that resolvers be capable of using
multiple source ports at once is arguably a new requirement, and could
have inter operation effects.
See:
http://ops.ietf.org/lists/namedroppers/namedroppers.2008/msg00873.html

As for the TCP fallback there is some concern in the operating community
that extensive use of TCP by resolver may cause problems. The chairs and
editors point out that TCP is an allowed transport protocol thus recommending
its use in certain situations, in particular when under attack is justified.


5) How solid is the WG consensus behind this document?  Does it
     represent the strong concurrence of a few individuals, with others
     being silent, or does the WG as a whole understand and agree with
     it?


The consensus is strong, on the document as whole.

6) Has anyone threatened an appeal or otherwise indicated extreme
     discontent?  If so, please summarize what are they upset about.

No one has threatened an appeal.


7) Have the chairs verified that the document adheres to _all_ of the
     ID nits?  (see http://www.ietf.org/ID-nits.html).

Yes but see note #1 above.


8) For Standards Track and BCP documents, the IESG approval
     announcement includes a write up section with the following
     sections:

     - Technical Summary

     DNS uses UDP for most of its query resolution process, to protect against
     forged UDP replies DNS has relied on a Query-ID field that is 16 
bits long.
     The size of this field was adequate when network connections 
were slower than
     is common today. The document documents measures to extend the effective
     Query-ID by using all available UDP ports, different source address (when
     possible) and using different authorative servers.


     All of the measures documented in the document, have been in use 
in certain
     implementations for a long time, and recently been almost universally
     deployed in all major implementations.

     - Working Group Summary

     There is a broad consensus that this important document be published.

     - Protocol Quality

     The techniques described in the document have been implemented 
and are in use
     use by number of implementations, with no interoperabilty 
issues. The only issues
     observed have been related to inability to allocate large number 
of open ports on
     certain operating systems, and firewalls/IDS not expecting the use of
     random ports by DNS resolvers.

       Olafur & Andrew


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Subject: Re: Defining defense levels...
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Ted Lemon wrote:

> There are still ways to forge the contents of a DNS zone.   But they  
> all involve getting access to the signing key for that zone.

Wrong.

A forged signature in an ancestor zone of the target zone is
enough.

The ancestor zone is the place upon where a trivial MitM attack
works.

> So yes, DNSSEC is not a panacea.

For fair evaluation of DNSSEC, let's accept your statement that:

>> I think you're seriously discounting the importance of human factors
>> when you say that the security of the DNS channel doesn't matter.

Now, you can see that human factors of DNSSEC channel through zones
does matter.

So, we can agree that PKIs, including DNSSEC, is seriously
discounting the importance of human factors.

With the agreement, the only thing we can do is to accept that
human management of DNS, including DNSSEC, is not very secure.

							Masataka Ohta


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Subject: Re: Zone Immortality
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Mark Andrews wrote:
>> RFC 1034 states:
>>
>>     Each secondary server is required to perform the following operations
>>     against the master, but may also optionally perform these operations
>>     against other secondary servers.  This strategy can improve the transfer
>>     process when the primary is unavailable due to host downtime or network
>>     problems, or when a secondary server has better network access to an
>>     "intermediate" secondary than to the primary.
>>
>>       
>>
>> Now, disregarding the obsolete "secondary" language (we now call them 
>> "slaves"), and the obviously-incorrect word "following" (which can't 
>> possibly be right, since this is the last paragraph of the section -- 
>> there is nothing relevant "following"), one notes the blatant ambiguity 
>> of "these operations". Which operations? Minimally, checking the serial 
>> number and performing a zone transfer if it has increased? I think that 
>> much is fairly obvious.
>>
>> What's a little *less* obvious, and the point of my missive, is whether, 
>> when and/or how "these operations" might include the following, from a 
>> previous paragraph: "
>>
>> If the secondary finds it impossible to perform a serial check for the EXPIRE
>>  interval, it must 
>> assume that its copy of the zone is obsolete an[sic] discard it."
>>
>> The problem with slaves resetting their EXPIRE timers every time they 
>> perform a successful refresh from another slave is that the slaves may 
>> be in a reciprocal or circular -- A refreshes from B, B refreshes from 
>> C, C refreshes from A -- relationship, so the zone may become 
>> "immortal", i.e. even when it is deleted from the primary master, the 
>> slaves continue to keep the zone alive indefinitely by constantly 
>> refreshing each other.
>>
>> Surely it cannot have been the intent for zones to become "immortal". 
>> That would defeat the whole purpose of having EXPIRE in the first place.
>>
>> Yet, having slaves in a reciprocal or circular relationship is a 
>> perfectly _valid_ arrangement. It ensures that, if the primary master 
>> goes down for an extended period of time (i.e. multiple REFRESH cycles), 
>> all slaves in the set eventually converge on the latest-available 
>> version of the zone.
>>
>> I would suggest, therefore, that if this language in 1034 cannot or will 
>> not be clarified/updated in the foreseeable future, so as to outlaw this 
>> "optional" replication topology, that implementors review their 
>> refresh/expire logic, and if it doesn't already exist in their 
>> implementation, provide a way for administrators to differentiate true 
>> "master" replication sources, which reset the EXPIRE timer on each 
>> successful refresh, from "peer"  sources, which do not. This would allow 
>> large enterprises --such as ours -- to build highly robust and available 
>> DNS infrastructures without having to struggle with zone-immortality 
>> risks/issues.
>>
>>                                                                          
>>                   - Kevin
>>     
>
> 	There are lots of existing ways to address this.
>
> 	* Outlaw loops.
> 	* Don't reset the expire counter on refresh from peers only
> 	  on transfer from peers.
>
> 	* Use DNSSEC to make data go stale.
>
> 	Extend AXFR/IXFR/SOA to add a expiry counter.  The master would
> 	always set this to SOA EXPIRE.  The slave would report it's
> 	current value for that counter.
>
> 	This fits well into EDNS as it is a hop-by-hop value.
>
> 	It would also address the N * expiry problem that currently
> 	exists when you have a deep transfer graph.
>
> 	e.g.  <EXPIRE><4><COUNTER>
>
> 	The slave would add a <EXPIRE><0> option to its SOA
> 	refresh queries and to IXFR and AXFR queries.
>
> 	The slave would use the maximum of the returned value and
> 	it's expire counter on SOA serial matches to refresh queries
> 	or IXFR up to date responses to set its expire counter.
>
> 	The slave would use this value rather than the SOA expire
> 	field to initialise it's expire counter on IXFR/AXFR which
> 	change the zone content.
>
> 	The slave will perform a sanity check to ensure that the
> 	returned value is no greater than the SOA expire field.  If
> 	it is greater then it will use the SOA expire field instead.
>   
I wasn't really angling to have a new protocol extension added, just 
pointing out an ambiguity in the spec, cautioning implementors as to the 
consequences of not carefully dealing with the ambiguity, and putting 
out one suggestion for how implementors could give administrators a way 
to avoid the immortality problem.

Your option "Don't reset the expire counter on refresh from peers only 
on transfer from peers" sounds like a slightly-more-fleshed-out version 
of what I was proposing ("differentiat[ing] true 'master' replication, 
which reset[s...] from 'peer' sources, which do not"). Thus, I approve 
:-). However it is formulated, the implementation would need to 
distinguish "peer" from "master".

Option "Outlaw loops" is simplest, in the Draconian sense, but as I 
think I explained in my original message, can be viewed as suboptimal, 
since it does not facilitate full convergence of all slaves during an 
extended outage of the master. Also, there is the question of how 
"outlaw loops" could be reliably enforced within the implementation, 
unless an overall management framework is assumed (and if such a 
framework is assumed, why not just assume, further, that the zone in 
question will be automatically deleted on all slaves when it is deleted 
on the master, thus rendering EXPIRE pointless and mooting the problem).

I can't comment intelligently on the DNSSEC solution, since, 
confessedly, I'm still somewhat of a DNSSEC neophyte. But, does the 
concept of "expire" in DNSSEC run parallel to the usual EXPIRE mechanism 
of "classical" DNS? Or does it override it?

As for the "expiry counter" idea, I like it, but to be perfectly honest, 
I don't know that either the immortality problem, or the N*EXPIRE issue, 
or both, can generate enough enthusiasm to get any traction for a 
protocol extension, at this time (given the other pressing DNS-security 
concerns at the moment).

                                                                         
               - Kevin


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From owner-namedroppers@ops.ietf.org  Mon Aug 25 22:05:15 2008
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To: Kevin Darcy <kcd@chrysler.com>
Cc: namedroppers@ops.ietf.org
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: Zone Immortality 
In-reply-to: Your message of "Mon, 25 Aug 2008 23:56:33 -0400."
             <48B37EF1.2080206@chrysler.com> 
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> As for the "expiry counter" idea, I like it, but to be perfectly honest, 
> I don't know that either the immortality problem, or the N*EXPIRE issue, 
> or both, can generate enough enthusiasm to get any traction for a 
> protocol extension, at this time (given the other pressing DNS-security 
> concerns at the moment).
> 
>                - Kevin

	The draft to describe this is written and posted.

	draft-andrews-dnsext-expire-00.txt

	Mark
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From: Ted Lemon <Ted.Lemon@nominum.com>
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Subject: Re: Defining defense levels...
Date: Mon, 25 Aug 2008 23:17:46 -0700
References: <61C362F7-2F64-49E6-8207-D586A9E5C101@icsi.berkeley.edu> <7365DD04-80AE-4B92-A7E9-B42D1C5CF649@nominum.com> <605121B6-0D01-4F79-BF07-5C6FA5F2A845@ICSI.Berkeley.EDU> <EE9E7140-C30D-462F-B413-62265B567245@nominum.com> <85BEB333-AD22-4571-9CB9-D1A45B868E38@ICSI.Berkeley.EDU> <C9F56D95-CF8F-4BC3-94FA-8C3B550B8388@nominum.com> <3C41C8BE-905A-46BD-9A18-A2186108A612@ICSI.Berkeley.EDU> <2FEBFB9F-43B7-465D-95D8-6E73ACFD64E9@nominum.com> <48B2AA2F.60805@necom830.hpcl.titech.ac.jp> <1D346610-B056-4148-B4AF-786311A38613@nominum.com> <48B346A8.1080708@necom830.hpcl.titech.ac.jp>
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On Aug 25, 2008, at 4:56 PM, Masataka Ohta wrote:
> Ted Lemon wrote:
>
>> There are still ways to forge the contents of a DNS zone.   But they
>> all involve getting access to the signing key for that zone.
>
> Wrong.
>
> A forged signature in an ancestor zone of the target zone is
> enough.
>
> The ancestor zone is the place upon where a trivial MitM attack
> works.

Right.   If you get the signing key for .com, you can forge anything  
under .com. If you get the signing key for fugue.com, you can sign  
anything under fugue.com.   And if you get the CA signing key one of  
the major CAs, you can generate new certs for whatever bank you want  
to spoof.

Right now, there simply isn't any protection against forged DNS  
information.

So DNSSEC is not a panacea, and certainly anybody who is running a  
zone that acts as a trust anchor for important zones below it should  
have a security policy that's appropriate for the level of trust being  
invested in them.

But this has nothing to do with the human factors argument I brought  
up, so I'm not sure why you mention it.   I don't think there is  
anybody on this mailing list at this point who does not understand how  
zones are signed, or what trust anchors do.

My point about human factors is that if you can make it much harder to  
forge a domain name, then this makes a lot of security downgrade  
attacks based on human factors (that is, tricks) much harder to carry  
out.


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From owner-namedroppers@ops.ietf.org  Tue Aug 26 07:01:06 2008
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> My belief is that there should be an official server with this  property. 
> Thus resolvers can query the server a few times on startup  to know if the 
> port number is preserved.  [1]

My laptop computer can be be connected via different firewalls during the 
course of the day.
The cache can be left running for weeks on end ( I reboot maybe once a 
month ).
I don't know if it is possible for the software to reliably detect that the 
nature of the connection has changed.

> But there are some anomalous servers, which for the same repeated  query 
> will return different values.  With this policy an anomalous  server which 
> returns different values for the same query will not be  cached yet will 
> be resolved by the client.  Cool beans: You punish  them with more load, 
> but their results still work.

Even though different values may be returned, assuming the number of valid 
results is finite (and not too large) [1], suitable confidence will be 
obtained. As an example, suppose there are 50 valid IP addresses, and the 
server returns a random subset of 8 of these on each query. After 7 queries 
at least one will have been returned twice, after 13 queries at least one 
will have been returned 3 times etc.

There is a problem though : deciding when the process has "converged". The 
simplest approach is to stop as soon as any result is available with 
required confidence value. This could result in the client being given just 
1 IP address, leading to an unexpected loss of resilience [2].

As an end user, I'm happy to live with this. I am doubtful that these 
anamolous servers are significant, and the example given seems quite 
artificial. If anyone knows differently, that would be interesting.

For such servers, an alternative would be to divide the 50 servers into 
groups ( 6 groups of 7 and one of 8 ), and then return a randomly selected 
group on each query. That ensures that a full set of at least 7 servers will 
be returned to the clients using a repeated query strategy.

 I'm also thinking about whether a more robust method of testing for 
convergence makes sense - for example sending extra queries if the result 
set shows unusual convergence - normally all confidence values will be 
equal. It seems to be hard however to distinguish between poor convergence 
and a possible attack with certainty.

[1] This assumption seems entirely reasonable to me.

[2] Many applications don't properly use multiple results, so the loss may 
be not be significant in any case.



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Date: Tue, 26 Aug 2008 06:56:08 -0700
From: Eric Rescorla <ekr@networkresonance.com>
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	"namedroppers@ops.ietf.org WG" <namedroppers@ops.ietf.org>
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At Mon, 25 Aug 2008 23:17:46 -0700,
Ted Lemon wrote:
> My point about human factors is that if you can make it much harder to  
> forge a domain name, then this makes a lot of security downgrade  
> attacks based on human factors (that is, tricks) much harder to carry  
> out.

I'm sorry but, I still don't understand this argument, since many
of the human factors tricks against TLS depend on getting the
user to override the mechanical checks. Are you arguing that
DNSSEC doesn't permit that kind of override or something else?

-Ekr



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To: "W.C.A. Wijngaards" <wouter@nlnetlabs.nl>
Cc: Namedroppers <namedroppers@ops.ietf.org>
Subject: Re: resolver side mitigation
References: <48B29A74.8020205@nlnetlabs.nl>
From: Florian Weimer <fweimer@bfk.de>
Date: Tue, 26 Aug 2008 16:23:36 +0200
In-Reply-To: <48B29A74.8020205@nlnetlabs.nl> (W. C. A. Wijngaards's message of "Mon, 25 Aug 2008 13:41:40 +0200")
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* W. C. A. Wijngaards:

> I've submitted a draft with the resolver side mitigations that I
> envision for Unbound.
>
> http://www.ietf.org/internet-drafts/draft-wijngaards-dnsext-resolver-side=
-mitigation-00.txt

I think RTT banding with 200 ms does not work that well if the
attacker is less than 200 ms away from the resolver which is attacked:
Suppose that NS1 has got a RTT of 20 ms, and NS2 one of 220 ms, and
the attacker is very close to the resolver (negligible RTT).  The
attacker sends a query to the resolver, initially spoofing responses
from both resolvers.  If no answer is received within 20 ms, it
concentrates spoofing on the other resolver.  As a result, the
necessary attack bandwidth has been reduced, leading to a better
attack.

In the end, the question whether RTT banding is useful boils down to
how we measure attack costs.  Without proper cost metrics, it's hard
to tell if a countermeasure is a real improvement (and how it
interacts with other resolver features like lameness caches).

Section 3.3 could mention that these techniques stop query mining
attacks on DNSSEC (because an off-path attacker cannot proxy DNSSEC
traffic anymore).  The downside is that when you detect a failure
(even if it's just a timeout), you need to back up, maybe even back to
the root, in order to get a fresh version of the data you've just
invalidated.  (I don't think this should be a priority item, though.)

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=DFe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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-----BEGIN PGP SIGNED MESSAGE-----
Hash: SHA1

Florian Weimer wrote:
> In the end, the question whether RTT banding is useful boils down to
> how we measure attack costs.  Without proper cost metrics, it's hard
> to tell if a countermeasure is a real improvement (and how it
> interacts with other resolver features like lameness caches).

Well, time to infection. Or is bandwidth better?
If the attacker does not determine what nameserver is being used, 2x in
the case above.  If smart, like you describe, about 1.1x (1/10 of the
time it has to use double bandwidth).  If the resolver sticks to the
fastest nameserver: 1x.

> Section 3.3 could mention that these techniques stop query mining
> attacks on DNSSEC (because an off-path attacker cannot proxy DNSSEC
> traffic anymore).  The downside is that when you detect a failure
> (even if it's just a timeout), you need to back up, maybe even back to
> the root, in order to get a fresh version of the data you've just
> invalidated.  (I don't think this should be a priority item, though.)

I do not understand what you mean with query mining.

If the NS or nameserver address query fails, simply give up on it.  Do
not back up to higher servers.  When the next query for this bailiwick
comes along, you'll get to the same spot again, and try again.

Best regards,
   Wouter
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From owner-namedroppers@ops.ietf.org  Tue Aug 26 07:58:19 2008
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To: "W.C.A. Wijngaards" <wouter@nlnetlabs.nl>
Cc: Namedroppers <namedroppers@ops.ietf.org>
Subject: Re: resolver side mitigation
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From: Florian Weimer <fweimer@bfk.de>
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* W. C. A. Wijngaards:

> Florian Weimer wrote:
>> In the end, the question whether RTT banding is useful boils down to
>> how we measure attack costs.  Without proper cost metrics, it's hard
>> to tell if a countermeasure is a real improvement (and how it
>> interacts with other resolver features like lameness caches).
>
> Well, time to infection. Or is bandwidth better?

Or packet count?  Or traffic volume?  It's not an easy answer, and
there are certainly lots of different trade-offs.

>> Section 3.3 could mention that these techniques stop query mining
>> attacks on DNSSEC (because an off-path attacker cannot proxy DNSSEC
>> traffic anymore).  The downside is that when you detect a failure
>> (even if it's just a timeout), you need to back up, maybe even back to
>> the root, in order to get a fresh version of the data you've just
>> invalidated.  (I don't think this should be a priority item, though.)
>
> I do not understand what you mean with query mining.

Spoofing the delegation while returning correct data, to get an
insight into which DNS data the victim is interested in.

> If the NS or nameserver address query fails, simply give up on it.  Do
> not back up to higher servers.  When the next query for this bailiwick
> comes along, you'll get to the same spot again, and try again.

But this doesn't deal with the situation that you keep querying the
wrong name server set, does it?

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=DFe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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From owner-namedroppers@ops.ietf.org  Tue Aug 26 08:12:22 2008
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On Aug 26, 2008, at 7:23 AM, Florian Weimer wrote:

> * W. C. A. Wijngaards:
>
>> I've submitted a draft with the resolver side mitigations that I
>> envision for Unbound.
>>
>> http://www.ietf.org/internet-drafts/draft-wijngaards-dnsext-resolver-side-mitigation-00.txt
>
> I think RTT banding with 200 ms does not work that well if the
> attacker is less than 200 ms away from the resolver which is attacked:
> Suppose that NS1 has got a RTT of 20 ms, and NS2 one of 220 ms, and
> the attacker is very close to the resolver (negligible RTT).  The
> attacker sends a query to the resolver, initially spoofing responses
> from both resolvers.  If no answer is received within 20 ms, it
> concentrates spoofing on the other resolver.  As a result, the
> necessary attack bandwidth has been reduced, leading to a better
> attack.
>
> In the end, the question whether RTT banding is useful boils down to
> how we measure attack costs.  Without proper cost metrics, it's hard
> to tell if a countermeasure is a real improvement (and how it
> interacts with other resolver features like lameness caches).


Actually, I think it does up the attacker work, just not by a full bit.

During the first 20ms, the attacker is sending as if from the "close"  
resolver, and then during the remaining 200ms of an epoc, from the  
"far" resolver..

If the attacker DOES have the feedback loop to know if there is  
immediate success and is "local" (0ms latency) and observing when the  
response comes back to determine that an attempt has failed.

If the resolver chose the "close" one, for the entire 20ms, none of  
the traffic is wasted. (no entropy gain), because the attacker starts  
a new race as soon as he observes the first one having failed.

If the resolver chose the "far" one, for the first 20ms, all the  
traffic is wasted, and for the remaining 200ms, the traffic is fully  
effective, which is still a gain in entropy but a far lower gain. (a  
less than 1b entropy gain, but still some gain).


If the attacker does NOT have the feedback loop, then it is a big gain  
in entropy:

If the resolver chose the "close" one, 200ms out of 220ms is wasted
If the resolver chose the "far" one, 20ms out of 220ms is wasted.

Thus I think if the attacker doesn't have the feedback loop, you still  
get a 1b gain in entropy (but not positive).


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From: Nicholas Weaver <nweaver@ICSI.Berkeley.EDU>
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On Aug 26, 2008, at 6:50 AM, George Barwood wrote:

>> My belief is that there should be an official server with this   
>> property. Thus resolvers can query the server a few times on  
>> startup  to know if the port number is preserved.  [1]
>
> My laptop computer can be be connected via different firewalls  
> during the course of the day.
> The cache can be left running for weeks on end ( I reboot maybe once  
> a month ).
> I don't know if it is possible for the software to reliably detect  
> that the nature of the connection has changed.

When it connects to a new firewall, you have an event where the  
network connectivity went down and up.  I imagine that on most systems  
this is a detectable event for your stub resolver.  (And how fixed are  
the stub resolvers anyway, vs the caching resolvers, in upping entropy  
at all?)


There are also other heuristics (eg, has the MAC for the gateway  
changed) which could also be used.

Additionally, although the resolving cache on your notebook is  
moderately important, where the NAT behavior is critical is on the  
centralized cache:  Far too many businesses with many systems put them  
all behind a NAT to save money and reduce exposure, as a NAT  
effectively acts as a one-way firewall.

It is these resolvers that need to be protected against NATs.


>> But there are some anomalous servers, which for the same repeated   
>> query will return different values.  With this policy an anomalous   
>> server which returns different values for the same query will not  
>> be  cached yet will be resolved by the client.  Cool beans: You  
>> punish  them with more load, but their results still work.
>
> Even though different values may be returned, assuming the number of  
> valid results is finite (and not too large) [1], suitable confidence  
> will be obtained. As an example, suppose there are 50 valid IP  
> addresses, and the server returns a random subset of 8 of these on  
> each query. After 7 queries at least one will have been returned  
> twice, after 13 queries at least one will have been returned 3 times  
> etc.

I'd still rather "don't bother":  Converging is going to be very long  
and a lot of traffic, probably far more than "just don't cache" at all  
for most cases.

And this is exactly why I believe in treating transactions vs caches  
separately: How many cases are there where you have "Race until win"  
on a transaction attack (vs getting something into the cache.   
Kaminski attacks are cache attacks)?

The only case I can come up with is cookie-hunting for insecure (non  
SSL-marked) cookies by generating a bunch of subdomains in iframes  
(bad1.login.yahoo.com, bad2.login.yahoo.com, etc) where the first one  
which succeeds will return the cookies to the attacker's server.

Can someone come up with other cases of blind transaction attacks?


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On Aug 26, 2008, at 6:56 AM, Eric Rescorla wrote:
> I'm sorry but, I still don't understand this argument, since many
> of the human factors tricks against TLS depend on getting the
> user to override the mechanical checks. Are you arguing that
> DNSSEC doesn't permit that kind of override or something else?

DNSSEC makes it harder to convince the browser to throw up a form that  
doesn't submit via SSL, or that submits to a different site via SSL.


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At Tue, 26 Aug 2008 08:26:52 -0700,
Ted Lemon wrote:
> 
> On Aug 26, 2008, at 6:56 AM, Eric Rescorla wrote:
> > I'm sorry but, I still don't understand this argument, since many
> > of the human factors tricks against TLS depend on getting the
> > user to override the mechanical checks. Are you arguing that
> > DNSSEC doesn't permit that kind of override or something else?
> 
> DNSSEC makes it harder to convince the browser to throw up a form that  
> doesn't submit via SSL, or that submits to a different site via SSL.

Well, I guess this is true, but I think it fixates on a specific
attack modality that isn't currently very important (hijacking) while
ignoring a modality that is currently very important (phishing).
DNSSEC doesn't do anything to stop either of the things you
mention when a phishing attack is in play.

Obviously, we're talking here about what can be done with DNS, but I
would observe that a set of browser mechanisms (e.g., PwdHash) that
reduced your risk from inadvertantly or maliciously being directed to
the wrong site would provide a significantly higher level of
protection against both classes of attack.

-Ekr


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On Aug 26, 2008, at 7:51 AM, Florian Weimer wrote:

> * W. C. A. Wijngaards:
>
>> Florian Weimer wrote:
>>> In the end, the question whether RTT banding is useful boils down to
>>> how we measure attack costs.  Without proper cost metrics, it's hard
>>> to tell if a countermeasure is a real improvement (and how it
>>> interacts with other resolver features like lameness caches).
>>
>> Well, time to infection. Or is bandwidth better?
>
> Or packet count?  Or traffic volume?  It's not an easy answer, and
> there are certainly lots of different trade-offs.

Packet counts == traffic volume to rough approximation.

And mitigations have different factors.

Entropy defenses is all about increasing the packet count required:  
making the probability of a win per packet being lower.

If there are cases, however, where an attacker can "run until win",  
entropy defenses don't affect time, but time*bandwidth product.  If  
you add one bit to the entropy, you either double the time the  
attacker needs or double the bandwidth required.



Cache policy is all about increasing the time required:  If there are  
no "run until win" cases, the packet count for an attack is not  
increased, but because of the attacker's inability to run multiple  
races for the same name within a single TTL, the number of races which  
can be run per unit time goes down, and with even short TTLs being  
60s, by a large amount.

Although its still a time*bandwidth problem, if the attacker doubles  
his bandwidth, the probability of winning any given race goes up, so  
fewer races need to be run to win, but time ends up dominating if the  
authority increases the TTL to 60 minutes.  Thus TTL is ONLY relevant  
as a defense if you can eliminate ALL "run until win" cases.


So my personal belief is "Packets, Time, and Time*Bandwidth" are all  
important criteria, and different defenses affect different portions,  
and we should be precise about which defenses affect which aspects of  
an attack.

>> If the NS or nameserver address query fails, simply give up on it.   
>> Do
>> not back up to higher servers.  When the next query for this  
>> bailiwick
>> comes along, you'll get to the same spot again, and try again.
>
> But this doesn't deal with the situation that you keep querying the
> wrong name server set, does it?

If you ALSO validate this when you put it in the cache for the first  
time, as well as anytime it changes, it should actually keep the wrong  
nameserver set from getting into the cache in the first place.

Basically, it works as follows.

If the attacker is doing a blind attack against the NS RRset set  
because its not yet in the cache, thats a "Run once every TTL" attack  
(conventional blind attack), which requires a LOT of time given the  
normal TTL on the NS RRset.


If instead, the attacker is doing a kaminski attack against the NS  
RRset, where he's taking advantage of trying to get the resolver to  
accept a change to the existing NS RRset, now the attacker doesn't  
have to win one race, he has to win two back-to-back races: one to  
make the resolver believe that the NS RRset has changed, which is  
immediately followed by a race where the resolver looks up the NS  
RRset again to see what the new value should be.


Yet at the same time, such a policy allows the NS RRset to  
legitimately change.


This is an example by what I mean about glue policy affecting the "run  
until win" property of a race:  With the policy of validating the NS  
RRset separately, you've changed the conditions from "Run until Win"  
to either "Run once every TTL" or "Run until win two races in a row"  
for attacks on the NS RRset: an exponentially harder problem.


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From: "George Barwood" <george.barwood@blueyonder.co.uk>
To: "Nicholas Weaver" <nweaver@ICSI.Berkeley.EDU>
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Subject: Re: Some Observations on Entropy Re: Some observations on dns-0x20
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> There are also other heuristics (eg, has the MAC for the gateway  changed) 
> which could also be used.

It all gets rather complex really, and complexity is enemy of security.
I might be connected via a mobile phone that keeps changing networks.
Or an intermediate local computer that uses multiple NAT connections.
Or all sorts of stuff that I have no idea about, or might happen in future.
[ Please understand I'm no expert in networking ]

> It is these resolvers that need to be protected against NATs.

Well there are more than a billion Windows computers, all wide open AFAIK.
No port randomization, no checking code, no repeat queries, nothing.
I'm not exactly sure how vulnerable they are in practice, but it doesn't 
feel good to me.

> I'd still rather "don't bother":  Converging is going to be very long  and 
> a lot of traffic, probably far more than "just don't cache" at all  for 
> most cases.

It's no bother really. It's a situation I don't expect in practice, but 
having something that will work (albeit with a second or two delay) if it 
ever does happen seems sensible.

> And this is exactly why I believe in treating transactions vs caches 
> separately: How many cases are there where you have "Race until win"  on a 
> transaction attack (vs getting something into the cache.   Kaminski 
> attacks are cache attacks)?

I haven't understood this concept. From my point of view being spoofed just 
once is unacceptable, if it can be defended. Besides, won't not caching 
opens up attacks?
But as I don't understand, maybe it's unwise to comment. 



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Subject: Re: Defining defense levels...
Date: Tue, 26 Aug 2008 09:30:19 -0700
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On Aug 26, 2008, at 9:04 AM, Eric Rescorla wrote:
> Obviously, we're talking here about what can be done with DNS, but I
> would observe that a set of browser mechanisms (e.g., PwdHash) that
> reduced your risk from inadvertantly or maliciously being directed to
> the wrong site would provide a significantly higher level of
> protection against both classes of attack.

I agree that the main opportunity to improve the situation is in the  
browser. However, that's a long-term effort.   DNSSEC is also a long- 
term effort, of course, but I have no idea which will bear fruit  
sooner, so I think it's prudent to work on both.  Neither will bear  
fruit if we just sit on our hands.


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At Tue, 26 Aug 2008 09:30:19 -0700,
Ted Lemon wrote:
> 
> On Aug 26, 2008, at 9:04 AM, Eric Rescorla wrote:
> > Obviously, we're talking here about what can be done with DNS, but I
> > would observe that a set of browser mechanisms (e.g., PwdHash) that
> > reduced your risk from inadvertantly or maliciously being directed to
> > the wrong site would provide a significantly higher level of
> > protection against both classes of attack.
> 
> I agree that the main opportunity to improve the situation is in the  
> browser. However, that's a long-term effort.   DNSSEC is also a long- 
> term effort, of course, but I have no idea which will bear fruit  
> sooner, so I think it's prudent to work on both.  Neither will bear  
> fruit if we just sit on our hands.

I don't believe I said we should just sit on our hands. I trust
you're not suggesting that I did.

-Ekr

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From owner-namedroppers@ops.ietf.org  Tue Aug 26 10:18:14 2008
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From: Nicholas Weaver <nweaver@ICSI.Berkeley.EDU>
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On Aug 26, 2008, at 9:19 AM, George Barwood wrote:

>> There are also other heuristics (eg, has the MAC for the gateway   
>> changed) which could also be used.
>
> It all gets rather complex really, and complexity is enemy of  
> security.
> I might be connected via a mobile phone that keeps changing networks.
> Or an intermediate local computer that uses multiple NAT connections.
> Or all sorts of stuff that I have no idea about, or might happen in  
> future.
> [ Please understand I'm no expert in networking ]

There are really two cases:  Either you're NATed (between you and the  
remote resolver/authority) or you aren't.

If you are NATed, port number offers NO entropy and NO protection,  
thus if you need entropy protection, and your default behavior is  
gaining it through port number, you MUST know if that protection is  
being stripped away.

Fortunately, not only is this easy to check, but (see below) easy to  
determine if its changed with very VERY high probability.

>> It is these resolvers that need to be protected against NATs.
>
> Well there are more than a billion Windows computers, all wide open  
> AFAIK.
> No port randomization, no checking code, no repeat queries, nothing.
> I'm not exactly sure how vulnerable they are in practice, but it  
> doesn't feel good to me.

Well, the stub resolvers can be trivially fixed with regard to cache  
attacks by simply removing the local cache from the stub resolver (or  
just setting the max TTL to a minute).

But that's cheating, and may have some bad properties.  (Note that it  
loads the recursive resolvers far more than it loads the rest of the  
infrastructure, as the union of the recursive resolvers' caches is a  
superset of the stub resolver's cache.).


More importantly: if your IP changes, your NAT state may have  
changed.  But if your IP doesn't change, the probability of the NAT  
state changing is very, VERY low.

Thus it is easy for a resolver to both determine if it is behind a NAT  
and if the status has changed.

The only case where this fails is if you move between two NATs that  
assign you the same IP address, but where the first NAT doesn't  
rewrite port numbers but the second NAT does, but a secondary  
heuristic of "If in the private address space, ASSUME I'm natted" is  
probably safe to trap these few cases.


So "Private IP?  Assume I'm natted.  Otherwise, IP changed?  Recheck  
for NAT" is a heuristic that should work very well for protecting the  
stub resolvers, and works great for the NATed recursive resolvers  
(which don't have the mobility issues, so you only need to check for  
NAT on startup).



>> I'd still rather "don't bother":  Converging is going to be very  
>> long  and a lot of traffic, probably far more than "just don't  
>> cache" at all  for most cases.
>
> It's no bother really. It's a situation I don't expect in practice,  
> but having something that will work (albeit with a second or two  
> delay) if it ever does happen seems sensible.

Unfortunately, it is "common enough"  from what I understand, but no  
evidence for myself.  :(

>> And this is exactly why I believe in treating transactions vs  
>> caches separately: How many cases are there where you have "Race  
>> until win"  on a transaction attack (vs getting something into the  
>> cache.   Kaminski attacks are cache attacks)?
>
> I haven't understood this concept. From my point of view being  
> spoofed just once is unacceptable, if it can be defended. Besides,  
> won't not caching opens up attacks?

Some observations:

1) In the blind attack, the attacker is the one generating the  
requests (through some mechanism) as well as the responses.

2) In ALL kaminski variants, and in MOST cases for traditional blind  
cache poisoning, the attacker really doesn't care about the result  
being returned, only that the result is CACHED for subsequent lookups,  
because the attacker generated the lookup in the first place!

In fact, it is the process of CACHING that opens up to all the glue  
poisoning/cache poisoning attacks.  If you don't have a cache at all,  
you can't have cache poisoning!


This is why I believe it is critical to separate out the notion of  
"Transaction" attacks from "cache" attacks.

In a blind transaction attack, the attacker ONLY needs to get you to  
accept the spoofed result for the current transaction.

But such cases are rare, because the attacker must trick the victim  
into making the request AND acting on the request in a way which harms  
the victim: the only case I can come up with is cookie-stealing from  
badly secured web-apps, but such webapps are weak to CookieMonster,  
Sidejacking, and other attacks.

In a blind cache attack, the attacker MUST get you to accept the  
spoofed result into the cache, but in return, the attacker only needs  
to trick the resolver into making the requests.


Thus although I agree that we need to protect both, if, due to  
circumstances (eg, NAT) where we can only protect one at the cost to  
the other, it may be a worthwhile tradeoff.



> But as I don't understand, maybe it's unwise to comment.

a)  I never let MY IGNORANCE stop me from commenting.  Why should  
anybody else?

b)  I believe the position I'm expounding SHOULD be clearly  
explainable.  If it doesn't make sense to you, its not a failure on  
your part, but a failure on my part!


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From: "George Barwood" <george.barwood@blueyonder.co.uk>
To: <namedroppers@ops.ietf.org>
Subject: Treatment of Bad IDs in entropy calculation
Date: Tue, 26 Aug 2008 18:57:09 +0100
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I just realised that Bad IDs can be neatly fitted into the entropy =
discounting mechanism I described earlier

( http://ops.ietf.org/lists/namedroppers/namedroppers.2008/msg01439.html =
).

The idea is to take into account the observed rate at which we are being =
attacked.

After computing the amount of entropy as before, we subtract Log2( =
BadIdCount ), where BadIdCount is the number of incorrect IDs observed =
while waiting for a response to the query.

For example:

ID =3D 16 bits
0x20 =3D 13 bits ( wWw.eXAmPle.Com )
200 Bad IDs seen =3D 8 bits

Effective entropy =3D 16 + 13 - 8 =3D 21 bits.

Dos ( denial of service ) can still occur if the attacker is sending =
enough spoof packets, so that effective entropy is reduced to zero, but =
if he can only spoof at moderate rates ( say a few thousand to the =
correct port per second ), resolution can still occur, albeit with extra =
requests.

Can anyone see a problem with this? It seems quite elegant to me.

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	charset="iso-8859-1"
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<!DOCTYPE HTML PUBLIC "-//W3C//DTD HTML 4.0 Transitional//EN">
<HTML><HEAD>
<META http-equiv=3DContent-Type content=3D"text/html; =
charset=3Diso-8859-1">
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<STYLE></STYLE>
</HEAD>
<BODY bgColor=3D#ffffff>
<DIV><FONT face=3DArial size=3D2>I just realised that Bad IDs can be =
neatly fitted=20
into the entropy discounting mechanism I described earlier</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>( <A=20
href=3D"http://ops.ietf.org/lists/namedroppers/namedroppers.2008/msg01439=
.html">http://ops.ietf.org/lists/namedroppers/namedroppers.2008/msg01439.=
html</A>&nbsp;).</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>The idea is to&nbsp;take into account =
the observed=20
rate at which we are being attacked.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>After computing the amount of entropy =
as before, we=20
subtract Log2( BadIdCount ), where BadIdCount is the number of incorrect =
IDs=20
observed while waiting for a response to the query.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>For example:</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>ID =3D 16 bits</FONT></DIV>
<DIV><FONT face=3DArial size=3D2>0x20 =3D 13 bits ( <A=20
href=3D"http://www.eXAmPle.Com">wWw.eXAmPle.Com</A> )</FONT></DIV>
<DIV><FONT face=3DArial size=3D2>200 Bad IDs seen =3D 8 =
bits</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>Effective entropy&nbsp;=3D 16 + 13 - 8 =
=3D 21=20
bits.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>Dos ( denial of service ) can still =
occur if the=20
attacker is sending enough spoof packets, so that effective entropy is =
reduced=20
to zero, but if he can only spoof at&nbsp;moderate rates ( say a few =
thousand to=20
the correct port per second ), resolution&nbsp;can still occur, albeit =
with=20
extra requests.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>Can anyone see a problem with this? It =
seems quite=20
elegant to me.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV></BODY></HTML>

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From owner-namedroppers@ops.ietf.org  Tue Aug 26 12:18:21 2008
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From: Evan Hunt <Evan_Hunt@isc.org>
To: George Barwood <george.barwood@blueyonder.co.uk>
Cc: namedroppers@ops.ietf.org
Subject: Re: Treatment of Bad IDs in entropy calculation
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> After computing the amount of entropy as before, we subtract
> Log2( BadIdCount ), where BadIdCount is the number of incorrect IDs
> observed while waiting for a response to the query.

Interesting thought.  Why log2(), exactly?  I'm not objecting, just not
quite sure I follow your reasoning.  I guess it's "we've gotten 256 bad
packets, so let's make it 256 times harder to guess"--but why not 512, or
1024, or a million?

Are you thinking of BadIdCount as counting incorrect responses for *all*
pending queries, or just for race that's currently being run?

-- 
Evan Hunt -- evan_hunt@isc.org
Internet Systems Consortium, Inc.

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From owner-namedroppers@ops.ietf.org  Tue Aug 26 13:19:55 2008
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Subject: Re: Treatment of Bad IDs in entropy calculation
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>> After computing the amount of entropy as before, we subtract
>> Log2( BadIdCount ), where BadIdCount is the number of incorrect IDs
>> observed while waiting for a response to the query.
>
> Interesting thought.  Why log2(), exactly?  I'm not objecting, just not
> quite sure I follow your reasoning.  I guess it's "we've gotten 256 bad
> packets, so let's make it 256 times harder to guess"--but why not 512, or
> 1024, or a million?

At a trivial level, it's simply that probabilities are being computed in the 
log space ( or some similar jargon ). This seems reasonable, as high 
precision is not required.

To try to be more explicit:

Suppose I calculate the entropy for a single query / response to be 29 bits.

This is intended to mean that an attacker has only a 1 in 2^29 chance of 
spoofing the response.

If the attacker is using multiple guesses, then clearly his odds are 
improved by that factor.

The nice part is that his multiple guesses can be easily seen, and the 
appropriate adjustment made, so that the calculated effective entropy is 
still realistic.

> Are you thinking of BadIdCount as counting incorrect responses for *all*
> pending queries, or just for race that's currently being run?

Just for the race that is currently being run.



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        namedroppers@ops.ietf.org
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: Some Observations on Entropy Re: Some observations on dns-0x20 
In-reply-to: Your message of "Tue, 26 Aug 2008 10:09:29 MST."
             <E5BE5763-4317-448B-ABF0-6D4E8DDA8C23@ICSI.Berkeley.EDU> 
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> 
> On Aug 26, 2008, at 9:19 AM, George Barwood wrote:
> 
> >> There are also other heuristics (eg, has the MAC for the gateway   
> >> changed) which could also be used.
> >
> > It all gets rather complex really, and complexity is enemy of  
> > security.
> > I might be connected via a mobile phone that keeps changing networks.
> > Or an intermediate local computer that uses multiple NAT connections.
> > Or all sorts of stuff that I have no idea about, or might happen in  
> > future.
> > [ Please understand I'm no expert in networking ]
> 
> There are really two cases:  Either you're NATed (between you and the  
> remote resolver/authority) or you aren't.
> 
> If you are NATed, port number offers NO entropy and NO protection,  

	If you are NAT'd the port number MAY offer you no protection.
	There are NAT's which attempt to preserve port numbers and
	actually do a pretty good job of doing that.

	If you are NAT'd the NAT MAY provide protection for nameservers
	that do not randomize their source ports by randomising the
	source port as a side effect of the NAT process.

	There are also NAT's which serialize the ports and NAT's
	which only emit one port and potentially serialize the qid
	as well.

	The only thing you can say about NATs is because there is
	no standard they can be doing ANYTHING to the queries.  This
	is one of the reasons NAT's are a abomination that people
	should be working to remove as soon as possible.

	Mark

-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Tue Aug 26 19:26:11 2008
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Subject: Re: Treatment of Bad IDs in entropy calculation
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On Tue, Aug 26, 2008 at 06:57:09PM +0100, George Barwood wrote:

> I just realised that Bad IDs can be neatly fitted into the entropy discounting mechanism I described earlier
> 
> ( http://ops.ietf.org/lists/namedroppers/namedroppers.2008/msg01439.html ).
> 

In short: I suspect you are describing a variation of channel
capacity, or some measure of signal/noise.  (There are many valid
security applications of such measurements.)

Caveat: I'm still digesting the GbDns source.  I'd like to offer some
preliminary comments on your minimum entropy calculation, based on
your email in this forum.  Please correct me if I've missed your
point.

> The idea is to take into account the observed rate at which we are
> being attacked.

I think there are two (or more) ways to understand your minimum
entropy analysis:

  a) from a DNS operator's perspective, the minimum entropy is
     a potential distraction.  For some DNS operators, this is
     not as important as the discrete probability that a
     forged packet might match the {qid, sport, 0x20, etc.} 
     transaction tuple.  Let's use your example to explain:

> For example:
> 
> ID = 16 bits
> 0x20 = 13 bits ( wWw.eXAmPle.Com )
> 200 Bad IDs seen = 8 bits
> 
> Effective entropy = 16 + 13 - 8 = 21 bits.

     Generally, if there are 2^{N} possible unique transaction tokens,
     the naive probability of success is 200/(2^{N}) ... and much,
     much more if there's a birthday window, of course.   Precisely,
     the failure of such a poisoning attack is:

\[
  1-p(n) = \bar{p}(n) = \prod_{k=0}^{n-1} \left(1 - \frac{1}{N-k}\right)
\]

     But most DNS servers have long since implemented duplicate
     upstream query protection.  We can therefore use the simple
     fraction to emphasize independence: the 200st failure does not
     make the 201st guess any more likely to (independently) match a
     transaction ID (again: *assuming* there is no birthday window,
     which otherwise significantly reduces the transaction integrity.)

     Another perspective, one I suspect you're considering, is:

  b) From a channel capacity perspective, the bad guesses are
     divisive (log 2) of the total keyspace, exactly as you proposed.
     Attacks are 'noise' compared to 'signal' from messages.
     Your ratio is not exactly S/N (you did not provide a bandwidth
     dimension).  But otherwise, it's the right idea and (as we say in
     Georgia) "good enough for government work".

     Seriously though, this perspective is useful for high-level
     decisions, such as research monitoring, characterizing DNS
     poisoning attempts as a "signal/noise" problem, and the mutual
     information found in large numbers of DNS transactions and
     poisonings.  I.e., one might care about the macro-level
     performance of DNS messaging as a channel to plan a lower-bound.

     A simple example: I might not make an embedded device that uses
     only 16 bits for TX tracking, based on minimum entropy analysis;
     I might instead consider the benefits of sport randomization
     (perhaps too expensive on my chosen platform), or 0x20 (variable,
     depending on the target users[0]), or some other protections.

     With a bandwidth dimension (not covered in minimum entropy
     analysis, AFAIK), one can perform this sort of risk analysis.

>  Can anyone see a problem with this? 

I think you'll encounter differences of opinion, depending on the
operator's perspective.  These may be expressed in terms that range
from sympathetic/appreciative to unhelpful/cynical.  But your general
S/N analysis (bandwidth and minimum entropy) is quite useful for
lower-bound estimation, I think.

Disagreement will depend on values: Local administrators will want
assurances that each malicious response has a low discrete probability
of being successful.  Network architects (particularly those realistic
about DNSSEC deployment, or facing hardware barriers for sport
adoption), will appreciate a S/N analysis.

In some networks, the need for improved security is measurably more
urgent, based on your minimum entropy analysis.  The solutions may
include not only sport randomization, but 0x20 encoding, DNSSEC,
stealthy forwarding, rfc 2181 gymnastics/policy, TCP fallback, etc.
Each solution has a cost, and may not be acceptable for everyone else,
or seen as anti-social if widely deployed.  

But you've proposed a way to measure the (bandwidth-adjusted)
benefit--one needs only compare this to costs.  I've not seen that
before; that's useful.

I don't know if I've described the differences in perspective
correctly.  I'd recommend reviewing the
'draft-wijngaards-dnsext-resolver-side-mitigation-00' document, which
seems to nicely capture much of the conversation Paul Vixie, Nick
Weaver and others have offered in this forum re: modality.

>  It seems quite elegant to me.

I agree; just add bandwidth (or point out where I've missed this).

I am still looking for a universal solution that satisfies the needs
of local admins ("make me secure; at all times; damn your numbers"),
and the oft-overlooked realities of large-scale DNS deployments
("locally clued users may be secure; but how can we herd 16M+ cats
into upgrading?")




[0] We've completed an overview of DNS-0x20, to appear at the CCS08
    conference:

     http://fritz.cc.gt.atl.ga.us/ccs08/ccs202-dagon.pdf

    We state: we find roughly ~12-16 bits; you found ~12.  This is a
    bias in any measurement, and there is no 'right' number, only
    densities.  Where one stops caring is a cost function, that
    you seem to propose.

-- 
David Dagon              /"\                          "When cryptography
dagon@cc.gatech.edu      \ /  ASCII RIBBON CAMPAIGN    is outlawed, bayl
Ph.D. Student             X     AGAINST HTML MAIL      bhgynjf jvyy unir
Georgia Inst. of Tech.   / \                           cevinpl."

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From owner-namedroppers@ops.ietf.org  Wed Aug 27 10:13:29 2008
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From: Andrew Sullivan <ajs@commandprompt.com>
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Subject: Protecting caches?
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No hat.

Dear colleagues,

In the discussion around forgery resilience so far, I've seen some
discussion on how to detect cache poisoning attempts, and some
discussion on how to foil the attack itself by reducing the ability of
the attacker to send bad data to a resolver.  (I've also seen the
observation, several times, that DNSSEC will solve these problems
anyway, so we should concentrate on deploying that; that's an
operational problem now, and not on-topic for this list.)  Some of the
proposals floated entail protocol (or maybe near-protocol --
"operational conventions", to borrow Joe Abley's nice phrase) changes,
and so are correctly on-topic for the WG.

What I haven't seen much of is discussion of protecting caches _as
such_.  That is, given that we are going to cache, are there
techniques that solve the dangers of a cache other than just
preventing the cache from ever having the wrong data in the first
place?  

Best regards,

A

-- 
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ajs@commandprompt.com
+1 503 667 4564 x104
http://www.commandprompt.com/

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From owner-namedroppers@ops.ietf.org  Wed Aug 27 10:13:51 2008
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From: Francis Dupont <Francis.Dupont@fdupont.fr>
To: Paul Vixie <vixie@isc.org>
cc: namedroppers@ops.ietf.org
Subject: Re: SCTP (and DCCP) 
In-reply-to: Your message of Sun, 24 Aug 2008 15:41:26 -0000.
             <71267.1219592486@nsa.vix.com> 
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 In your previous mail you wrote:

   > DCCP is younger but its "market" is far larger.
   
   by "larger" do you mean "number of flows now using it" or something else?

=> the potential market: SCTP was designed for SS7 and should replace TCP
extremely slowly, DCCP is for VoIP & co.

Regards

Francis.Dupont@fdupont.fr

PS: note I have been a fan of SCTP for many years. I am just old enough
to understand SCTP adoption should take at least a decade.

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From owner-namedroppers@ops.ietf.org  Thu Aug 28 08:00:40 2008
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Date: Thu, 28 Aug 2008 16:45:30 +0200
From: Stephane Bortzmeyer <bortzmeyer@nic.fr>
To: bert hubert <bert.hubert@netherlabs.nl>, namedroppers@ops.ietf.org,
	davidu@everydns.net
Subject: Re: EDNS PING first draft uploaded
Message-ID: <20080828144530.GA15926@nic.fr>
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On Sun, Aug 17, 2008 at 10:25:46PM +0200,
 bert hubert <bert.hubert@netherlabs.nl> wrote 
 a message of 36 lines which said:

> a draft which describes a very simple EDNS PING option.

Although you mention the DNS cookies proposal
(draft-eastlake-dnsext-cookies), you offer no rationale of why your
solution is "better". Unlike draft-reid-dnsext-aleatoric, which
follows a different path, EDNS ping seems so close of the cookies that
one can wonder why there are two proposals.

At first reading, the differences seem to be:

- EDNS ping may be simpler to implement

- the draft on EDNS ping is quite... drafty and, for instance, does
 not address downgrade attacks (compare with the use of "soft state"
 in cookies)

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From owner-namedroppers@ops.ietf.org  Thu Aug 28 08:14:50 2008
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Date: Thu, 28 Aug 2008 17:04:15 +0200
From: Stephane Bortzmeyer <bortzmeyer@nic.fr>
To: "W.C.A. Wijngaards" <wouter@nlnetlabs.nl>
Cc: Namedroppers <namedroppers@ops.ietf.org>
Subject: Re: resolver side mitigation
Message-ID: <20080828150415.GA18080@nic.fr>
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On Mon, Aug 25, 2008 at 01:41:40PM +0200,
 W.C.A. Wijngaards <wouter@nlnetlabs.nl> wrote 
 a message of 14 lines which said:

> I've submitted a draft with the resolver side mitigations that I
> envision for Unbound.
> 
> http://www.ietf.org/internet-drafts/draft-wijngaards-dnsext-resolver-side-mitigation-00.txt

>   o  source address randomisation
>
>      If the resolver has multiple public IP addresses these can be used
>      to randomise with.

With IPv4, this would add only one or two bits of entropy.

But, with IPv6, there is a huge potential for randomisation, may be 64
bits of entropy if the resolver has a full /64.

However, it has implications for the router's Neighbor Discovery
cache. Did anyone tried aggressive source address randomisation with
IPv6 to see until where the router and/or server OS can go?

> Specifically, they must not put the costs of the solution with 3rd
> parties.  

That's a noble goal but it is impossible to follow completely. For
instance:

>   o  Authority queries for nameserver addresses, A and AAAA.
>
>      Same idea, like NS query above.  You ask for A or AAAA records
>      directly at the authoritative server.  

This would increase the load of the authoritative servers and
therefore would put a part of the cost (an acceptable one, IMHO) on
third parties.


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From owner-namedroppers@ops.ietf.org  Thu Aug 28 08:42:44 2008
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On Wed, Aug 06, 2008 at 05:13:00PM +0100,
 Jim Reid <jim@rfc1035.com> wrote 
 a message of 38 lines which said:

> This idea is probably even uglier than the 0x20 draft. :-)

I like it although I'm not sure it is better than cookies: after all,
a name server software has to be changed in one way or the other. If
we are going to add AL support, why not directly adding cookies? AL
seems interesting only if EDNS support is unrealistic (too complicated
for the name server software or blocked by a stupid firewall). Is it a
sufficient motivation?

Also, you do not address downgrade attacks, apparently? How to know if
a response without AL comes from an old server, not upgraded, or from
an attacker?


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Subject: Stupid questions on stub resolvers...
Date: Thu, 28 Aug 2008 08:31:25 -0700
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Do people know of any stub resolvers which cache beyond the direct  
answer when asking a recursive resolver?

EG, if the recursive resolver when asked "www.foo.com", also returns  
an additional record "advertisements.foo.com A 12.34.56.78", will any  
known stub resolvers cache that additional value?



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From owner-namedroppers@ops.ietf.org  Thu Aug 28 08:56:27 2008
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Subject: Re: resolver side mitigation
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On Aug 28, 2008, at 8:04 AM, Stephane Bortzmeyer wrote:
>>  o  Authority queries for nameserver addresses, A and AAAA.
>>
>>     Same idea, like NS query above.  You ask for A or AAAA records
>>     directly at the authoritative server.
>
> This would increase the load of the authoritative servers and
> therefore would put a part of the cost (an acceptable one, IMHO) on
> third parties.

I've been looking at this myself, from a trace based viewpoint.

Some preliminary suggestion on the traces I have is that the MOST  
paranoid AND agressive policy (which I believe ends up being roughly  
equivelent to the new policy for Unbound):


+ Do not accept ANY data into the cache that was not a direct answer.

+ Deliberately fetch all data that wasn't a direct answer and isn't  
already in the cache independently to place in the cache.

Thus, eg, for the NS RRSet, it generates both a separate fetch for the  
NS RRSet, and a fetch for each name in that RRSet.

This policy increases the number of queries outbound from the  
resolvers by about 70-90%, so its less than double.

It would not increase the latency of queries however, except in the  
case of CNAME chains, assuming you are still able to use the glue  
records in the local context of an individual query.


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From owner-namedroppers@ops.ietf.org  Thu Aug 28 09:05:34 2008
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On 28 Aug 2008, at 16:27, Stephane Bortzmeyer wrote:

> AL seems interesting only if EDNS support is unrealistic (too  
> complicated
> for the name server software or blocked by a stupid firewall). Is it a
> sufficient motivation?

AL works (for some definition of work) regardless of EDNS support. So  
I suppose that is some sort of motiovation. Whether it's sufficient  
motivation is up to this WG to decide.

> Also, you do not address downgrade attacks, apparently? How to know if
> a response without AL comes from an old server, not upgraded, or from
> an attacker?

It doesn't handle downgrade attacks. So AL in its current incantation  
is flawed. OTOH, it does raise the barrier for cache poisoners.

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From owner-namedroppers@ops.ietf.org  Thu Aug 28 09:24:35 2008
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Subject: Re: Stupid questions on stub resolvers...
Date: Thu, 28 Aug 2008 09:15:17 -0700
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On Aug 28, 2008, at 8:31 AM, Nicholas Weaver wrote:
> Do people know of any stub resolvers which cache beyond the direct  
> answer when asking a recursive resolver?

If you've installed BIND:

% man lwresd

Regards,
-drc


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From owner-namedroppers@ops.ietf.org  Thu Aug 28 09:25:56 2008
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Date: Thu, 28 Aug 2008 12:17:08 -0400
From: Andrew Sullivan <ajs@commandprompt.com>
To: namedroppers@ops.ietf.org
Subject: REMINDER: rfc2672bis WGLC expiring!
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Dear colleagues,

We posted the WGLC for draft-ietf-dnsext-rfc2672bis-dname-14 on
2008-07-31.

The WGLC is due to close at 17:00 EDT today.

We have not had anywhere close to the five required reviewers for the
document say something about it.  (We had two comments on the -14
draft immediately after it was posted, to which the editors responded,
and no responses to the WGLC itself.  If the two people who responded
to the posting of the draft say that, apart from their one request,
they otherwise support sending the draft along, that would help, but
it would still leave us at least 3 short.)

If you have read the document and think it should be sent along for
the status of Proposed Standard, please post something to the list to
this effect.

If you have not read the document, and won't have time to do a review
prior to the close of the WGLC today, but _will_ commit to reviewing
the document in the near future (say, the next 7 days), please post
that to the list.  If we have interest in the document, and people
just haven't had time due to vacations or whatever, we can certainly
extend the LC a little longer.

Remember that, if the document does not get adequate review and
support, our convention requires that we do not send it along for
publication.  

Thanks,

Andrew (for the Chairs)

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Cc: Nicholas Weaver <nweaver@ICSI.Berkeley.EDU>,
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The problem I have with this proposal, and any proposal that requires  
both resolver and authority changes is as follows:

DNSSEC's major deployment problem is that it requires double-sided  
deployment: changes to both the resolver and authority to have an  
effect, thus in the case of partial deployment, only the intersection  
of changed-resolvers & changed-authorities sees a benefit.

Thus if a proposed mitigation for blind injection requires double- 
sided changes, why not just do DNSSEC, especially if you make it easy  
to DO DNSSEC?  Perhaps, by following the lead of some of SSH's  
usability hacks, just make it easy to do in a manner which is insecure  
to authority compromise.



This contrasts greatly with other methods of increasing entropy of  
cached entries: Port, address, and 0x20 randomization take advantage  
of how existing authorities work, so it requires only changes to the  
resolver.

Likewise, "duplicate and cache-on-agreement" will result in entropy  
increases to arbitrary values and the only cases where you fail to  
cache are ones where you get multiple return values for the same  
query, and as others have pointed out on the list, you could recurse  
until you get a converged entry appearing in multiple responses, so  
again, its a way of increasing entropy (to arbitrary limits, too!)  
that does not



The minor problem I have is there seems to be a discomfort with  
entropy: if you can get the query entropy to be over 40b for the  
purposes of caching, you can make blind attacks on the cache  
completely infeasible with just a single counter of bad responses: 10M  
packets to have a .001% chance of poisoning a single entry, and if you  
wipe the cache at that point, well, 10M packets to cause the cache to  
void 1M entries?  Hardly seems a DOS to me.

Especially if combined with cache policies on the resolver which  
eliminate all "Race until win" conditions.

And also "void on changed double-response" detection if you are  
willing to manage the outstanding state.



After all, blind attacks on TCP can be done as well:  Observe that  
these days, most systems don't actually respond to unsolicited packets  
with RSTs, so if the legit packets are received by the destination but  
the destination doesn't see the sequencing right, they will be  
ignored.  And even if not, if the attacker is closer than the legit  
destination, the legit RSTs will never be received.

Guess the sender's source port (predictible) and sequence number and  
respond with an appropriate SYN/ACK.  Then guess that they will do the  
DNS request, and send the response with the next in sequence + a FIN.

Thus instead of blindly sending individual packets with a random ID,  
you're sending a blind string of 3 packets (SYN/ACK, data, FIN) where  
you use random SEQ # and random TXID, with a tiny gap between the SYN/ 
ACK and the data to give the host time to process.

This is 16b entropy for the transaction ID, but 32b of entropy for  
initial sequence #, making it a 48b of entropy problem.  TCP, the  
"Ultimate fallback" is really just an easy way of adding 32b of  
entropy to a query: getting the query entropy to 48b.

Why isn't this done to attack other protocols?  Because attackers have  
better things to do than bang against the network on a 48b entropy  
problem.


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From owner-namedroppers@ops.ietf.org  Thu Aug 28 10:28:22 2008
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On 28 Aug 2008, at 17:51, Nicholas Weaver wrote:

> Thus if a proposed mitigation for blind injection requires double- 
> sided changes, why not just do DNSSEC, especially if you make it  
> easy to DO DNSSEC?

This is like saying let's solve world hunger by just giving everyone  
enough food: naive and not particularly helpful.

Deployment of DNSSEC is going to take a Long, Long Time, even with  
much improved tools. So what does the world do until then?

Ugly kludges like AL or 0x20 are relatively painless to deploy, so  
they can buy some breathing space until the root's signed, everyone's  
got DNSSEC-aware resolvers and there are plenty of decent tools to  
sign zones, manage keys and debug validation failures. In this  
context, "deploy" means nothing more than update your DNS software.  
Even when this isn't straightforward, it's still far easier than all  
the goop that has to go alongside updating DNS software to accommodate  
DNSSEC deployment: eg configure and maintain trust anchors, generate  
keys, change zone management tools/processes to incorporate signing,  
handle key rollover, etc, etc. It would be wonderful if these things  
could be reduced to close-to-zero effort.  But DNSSEC isn't like that.  
Sigh.



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From owner-namedroppers@ops.ietf.org  Thu Aug 28 10:37:55 2008
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From:	 JINMEI Tatuya / =?ISO-2022-JP?B?GyRCP0BMQEMjOkgbKEI=?=
 <Jinmei_Tatuya@isc.org>
To:	 Stephane Bortzmeyer <bortzmeyer@nic.fr>
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At Thu, 28 Aug 2008 17:04:15 +0200,
Stephane Bortzmeyer <bortzmeyer@nic.fr> wrote:

> > http://www.ietf.org/internet-drafts/draft-wijngaards-dnsext-resolver-side-mitigation-00.txt
> 
> >   o  source address randomisation
> >
> >      If the resolver has multiple public IP addresses these can be used
> >      to randomise with.
> 
> With IPv4, this would add only one or two bits of entropy.
> 
> But, with IPv6, there is a huge potential for randomisation, may be 64
> bits of entropy if the resolver has a full /64.
> 
> However, it has implications for the router's Neighbor Discovery
> cache. Did anyone tried aggressive source address randomisation with
> IPv6 to see until where the router and/or server OS can go?

I've not played with this idea yet, but if I were to do it, I would
reserve a separate /64 for the server machine, assign any addresses
under that prefix on some "loopback" interface (with disabling DAD),
and let the server announce the prefix for neighboring routers (and
have them accept the route).

---
JINMEI, Tatuya
Internet Systems Consortium, Inc.

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From owner-namedroppers@ops.ietf.org  Thu Aug 28 10:54:56 2008
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Andrew Sullivan wrote:
> Dear colleagues,
>
> We posted the WGLC for draft-ietf-dnsext-rfc2672bis-dname-14 on
> 2008-07-31.
>
> The WGLC is due to close at 17:00 EDT today.
>
> We have not had anywhere close to the five required reviewers for the
> document say something about it.  (We had two comments on the -14
> draft immediately after it was posted, to which the editors responded,
> and no responses to the WGLC itself.  If the two people who responded
> to the posting of the draft say that, apart from their one request,
> they otherwise support sending the draft along, that would help, but
> it would still leave us at least 3 short.)
>
> If you have read the document and think it should be sent along for
> the status of Proposed Standard, please post something to the list to
> this effect.
>
>   

I have read the document, and understand it. I am in favour of it 
advancing to Proposed Standard.

Brian Dickson

> If you have not read the document, and won't have time to do a review
> prior to the close of the WGLC today, but _will_ commit to reviewing
> the document in the near future (say, the next 7 days), please post
> that to the list.  If we have interest in the document, and people
> just haven't had time due to vacations or whatever, we can certainly
> extend the LC a little longer.
>
> Remember that, if the document does not get adequate review and
> support, our convention requires that we do not send it along for
> publication.  
>
> Thanks,
>
> Andrew (for the Chairs)
>
>   


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From owner-namedroppers@ops.ietf.org  Thu Aug 28 12:34:30 2008
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From: Paul Vixie <vixie@isc.org>
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Subject: kaminsky resistance, section by section
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the perfect platonic form of kaminsky's observation is that the target of
the poison does not have to match the q-tuple.  all else is a reflection of
that form, including ttl bypasses (ADNS which fails to answer unknown qtype,
middleboxes which block or drop unknown qtype, RDNS which fails to cache
some qtypes, etc), and no matter what is the form of the non-qtuple-matching
poison.  i've watched with interest as weaver, ohta, and others have explored
ways to protect against each known form of poison or to protect against any
form of non-qtuple-matching poison.  yesterday leo bicknell of ISC re-raised
a proposal that seemed to him related to dns-0x20 but wasn't, and which had
seemed to me earlier on to be "too partial" to be worth its deployment cost,
but the debates have swirled long enough now that i think there's "meat" here.

section by section, then, here's what we could do.  the header section is not
an issue since it contains only flags and metadata.  the question section is
not an issue since it can by universal convention only hold one q-tuple and
that q-tuple is both well understood and well extended by dns-0x20.  of the
other three sections there is much to say.  note in advance that nothing i'll
say removes the need for port randomization or DNSSEC, but i'm starting to be
of the opinion that (a) we don't have to live with the ten-hour attack, and
(b) we have more we must do while we complete the long march toward DNSSEC.

it's nec'y that the result of all transactions be cached, whether that
result was NXDOMAIN, NODATA, SERVFAIL, timeout, or live data.  failing to
cache the result of "this q-tuple from that ADNS", means that a given
q-tuple can be serially attacked.  it's also nec'y that multiple
simultaneous outstanding upstream transactions not be the result of
multiple simultanous cache misses from downstream queries, or else any
given q-tuple can be attacked in parallel.  caches must be deep enough to
hold at least several seconds of full rate churn, so that no q-tuple can be
attacked multiple times per second.

for the answer section it's essential that only records whose owners match
the q-tuple be cached or forwarded or consumed.  so, full cname chains, or
partial cname chains, whether apparently sharing a baliwick with the
q-tuple or not, are unusable.  it's no longer going to be possible to make
an authority server a stealth slave for some common CNAME destination and
try to cut down the number of round trips needed to complete a CNAME chain.

for the authority section we have the problems of fast flux, of poison, of
load balancers, and of legitimate NS RRset changes.  we must allow a
response to have the effect of changing the cached NS RRset, but we cannot
allow the kind of immediate+direct replacement that's been widely
implemented to date.  one non-immediate non-direct approach (proposed by me
and by others) is to reduce the TTL rather than replacing the RRset so as
to allow slow legitimate changes to cached NS RRsets but to ensure that
changes are validated through the parent zone somehow.  leo bicknell's
observation yesterday is that at the cost of one extra round trip per
delegation discovery we can separate the discovery of the delegation chain
from the discovery of the answer.  since we can hope that a delegation
chain will be used many times before it expires or is replaced, this is a
reasonable design cost.  therefore for any given q-tuple where we have no
specifically associated knowledge of its delegation chain, we can first ask
for <randomstring>.<qname> and iterate downward along the returned NS RRsets
until we receive one that isn't a delegation (indicating that "randomstring"
matches a wilecard, or until we receive an NXDOMAIN.  since there's no way
to be sure that www.<domain> and ftp.<domain> aren't zone apexes, we'll have
to ask for <random>.www.<domain> and <random>.ftp.<domain> separately, even
though we'll normally just learn that only <domain> has an NS RRset.  this
extra cost allows us to commit to a draconian NS RRset replacement strategy:
if a response contains an NS RRset which attempts to change the cache, then
simply ignore the new one and delete the cached one, and restart iteration.
(this policy isn't effective without bicknell's NS RRset discovery modality,
since the iteration we'd fall back to today, is predictable and vulnerable.)

for the additional section we have quite a lot of protection from RFC 2181
already.  kashpureff taught us a lot.  but even so we're currently capable
of inserting new RRsets into the cache which while "in baliwick" are at
least theoretically attached to poisoned MX or SRV or NS records in the
answer or authority section.  nothing i've said above about protecting the
other sections makes it safe to consume, cache, or reuse in-baliwick data
contained in the additional section.  ohta has long urged that we collapse
the data structure to remove the intermediate name (target of MX/SRV/NS,
owner of A/AAAA) and just associate addresses directly with the records that
need this kind of "glue".  weaver has recently made an observation which i
find compelling -- if one follows ohta's proposal only for the purpose of
making a direct query to that baliwick for the glue record in question, and
never let anything in the additional section affect the cache at all ever,
then we've closed this window.  but i'm only compelled by this proposal in
light of bicknell's observation (described earlier), such that the downquery
meant to retrieve this glue should begin with a <random>.gluename query in
order to complete the delegation chain through to the subzone's apex, after
which point a normal query for the gluename against that baliwick, with the
normal rules for caching only answers matching the q-tuple and disallowing
subsequent NS RRset replacement without first deleting and reaquiring that
link in the delegation chain.

this description is hard to follow, and frankly it was hard to write.  i'm
conjoining "things you have to do differently when you decide where to send
a query" with "things you have to do differently when you receive an answer"
and that makes a lot of people nervous.  but as you contemplate the anxiety
and complexity in this proposal, note that its approach is to try to decide
what CAN be cached, and not to try to decide what CAN'T be cached.

i ask that questions of the form "i don't understand" or "this makes no sense"
be sent to me personally rather than to the list -- i will then know what i
need to improve in the proposal and we can avoid compounded misunderstandings
that will make the evaluation of this take even longer than it must.

and note, again, that even if successful, this proposal doesn't reduce the
need for DNSSEC, since it only seeks to protect against off-path attacks, and
we all ought to continue to be very concerned about on-path attacks as well.

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>    If you are NAT'd the port number MAY offer you no protection.
>    There are NAT's which attempt to preserve port numbers and
>    actually do a pretty good job of doing that.
> 
>    If you are NAT'd the NAT MAY provide protection for nameservers
>    that do not randomize their source ports by randomising the
>    source port as a side effect of the NAT process.
> 
>    There are also NAT's which serialize the ports and NAT's
>    which only emit one port and potentially serialize the qid
>    as well.

Mark,

Can we please make a distinction between plain NATs (which only affect 
TCP/UDP and IP headers) and proxies (or ALGs) which manipulate the 
protocol at higher levels?

I've never seen a NAT which affects QIDs.  I've seen plenty of ALGs that 
do, though, many of which did indeed pick serial QIDs :(

Ray



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> Ugly kludges like AL or 0x20 are relatively painless to deploy, ...

don't mention these together, please.  0x20 is a one-side upgrade (RDNS only).

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meaning no disrespect to leo bicknell, a more careful review of my inbox
reveals that evan hunt, not leo bicknell, first told the idea of "prepend
random label to the qname until you're sure you know the entire delegation
chain", so in fairness to evan, i will change this attribution the next
iteration of the writeup of this.


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To: Ray.Bellis@nominet.org.uk
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: Some Observations on Entropy Re: Some observations on dns-0x20 
In-reply-to: Your message of "Thu, 28 Aug 2008 22:03:20 +0100."
             <OF5BF097B3.1CAAC6D8-ON802574B3.00727D44-802574B3.0073A9AD@nominet.org.uk> 
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> >    If you are NAT'd the port number MAY offer you no protection.
> >    There are NAT's which attempt to preserve port numbers and
> >    actually do a pretty good job of doing that.
> > 
> >    If you are NAT'd the NAT MAY provide protection for nameservers
> >    that do not randomize their source ports by randomising the
> >    source port as a side effect of the NAT process.
> > 
> >    There are also NAT's which serialize the ports and NAT's
> >    which only emit one port and potentially serialize the qid
> >    as well.
> 
> Mark,
> 
> Can we please make a distinction between plain NATs (which only affect 
> TCP/UDP and IP headers) and proxies (or ALGs) which manipulate the 
> protocol at higher levels?
> 
> I've never seen a NAT which affects QIDs.  I've seen plenty of ALGs that 
> do, though, many of which did indeed pick serial QIDs :(
> 
> Ray

	I agree with you that there is a difference.   The problem
	of course is that you often don't know that a ALG is also
	installed in the NAT box.

	You generally buy a NAT (router in some markets) and have
	no idea of what's inside as the vendors don't give you
	enough details.  You are also often not in a position to
	see the traffic on both sides as the upstream may be a
	cable/dsl modem and not ethernet.

	Mark
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Thu Aug 28 18:16:06 2008
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Subject: Re: Some Observations on Entropy Re: Some observations on dns-0x20 
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On Aug 28, 2008, at 5:04 PM, Mark Andrews wrote:
>
> 	I agree with you that there is a difference.   The problem
> 	of course is that you often don't know that a ALG is also
> 	installed in the NAT box.
>
> 	You generally buy a NAT (router in some markets) and have
> 	no idea of what's inside as the vendors don't give you
> 	enough details.  You are also often not in a position to
> 	see the traffic on both sides as the upstream may be a
> 	cable/dsl modem and not ethernet.

However, for purposes of building a DNS resolver, you can probe for  
the detailed behavior, including port, ID, IP, etc, by querying a  
properly constructed authority, so you can be in a position to see  
both sides of the traffic: you just have to ask somebody who will tell  
you the other side.

{port,txid,server}.{anything}.nettest.icir.org is one protoype example.

This works in all cases where the NAT/proxy is not malicious  
(deliberately whitelisting the tests) and who's behavior doesn't  
change (you can always repoll to check for changed behaviors at a  
reasonable interval, however).

For a malicious proxy in path, you are sunk however, but with a  
malicious proxy in path, you are sunk period.


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To: Nicholas Weaver <nweaver@ICSI.Berkeley.EDU>
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: Some Observations on Entropy Re: Some observations on dns-0x20 
In-reply-to: Your message of "Thu, 28 Aug 2008 18:06:55 MST."
             <0F6ADF3E-AB46-4C14-8588-A4D874FF2ADC@icsi.berkeley.edu> 
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> 
> On Aug 28, 2008, at 5:04 PM, Mark Andrews wrote:
> >
> > 	I agree with you that there is a difference.   The problem
> > 	of course is that you often don't know that a ALG is also
> > 	installed in the NAT box.
> >
> > 	You generally buy a NAT (router in some markets) and have
> > 	no idea of what's inside as the vendors don't give you
> > 	enough details.  You are also often not in a position to
> > 	see the traffic on both sides as the upstream may be a
> > 	cable/dsl modem and not ethernet.
> 
> However, for purposes of building a DNS resolver, you can probe for  
> the detailed behavior, including port, ID, IP, etc, by querying a  
> properly constructed authority, so you can be in a position to see  
> both sides of the traffic: you just have to ask somebody who will tell  
> you the other side.
> 
> {port,txid,server}.{anything}.nettest.icir.org is one protoype example.
> 
> This works in all cases where the NAT/proxy is not malicious  
> (deliberately whitelisting the tests) and who's behavior doesn't  
> change (you can always repoll to check for changed behaviors at a  
> reasonable interval, however).
> 
> For a malicious proxy in path, you are sunk however, but with a  
> malicious proxy in path, you are sunk period.
 
And one really wants a solution where you don't need to care about
whether the port or txid are being changed or not.  You also want
one where you can detect a malicious proxy / cache.

Mark
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Thu Aug 28 19:38:56 2008
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> > {port,txid,server}.{anything}.nettest.icir.org is one protoype example.
> > 
> > This works in all cases where the NAT/proxy is not malicious  
> > (deliberately whitelisting the tests) and who's behavior doesn't  
> > change (you can always repoll to check for changed behaviors at a  
> > reasonable interval, however).
> > 
> > For a malicious proxy in path, you are sunk however, but with a  
> > malicious proxy in path, you are sunk period.
>  
> And one really wants a solution where you don't need to care about
> whether the port or txid are being changed or not.  You also want
> one where you can detect a malicious proxy / cache.
> 
> Mark

agreed.  testing for this and responding to it adds complexity and doesn't
nec'ily buy you anything if the ADNS you're querying is behind their own
local NAT-based derandomizer.

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 00:03:42 2008
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To: Andrew Sullivan <ajs@commandprompt.com>
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Subject: Re: Protecting caches?
References: <20080827170822.GH18946@commandprompt.com>
From: Florian Weimer <fweimer@bfk.de>
Date: Fri, 29 Aug 2008 08:52:07 +0200
In-Reply-To: <20080827170822.GH18946@commandprompt.com> (Andrew Sullivan's message of "Wed, 27 Aug 2008 13:08:22 -0400")
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* Andrew Sullivan:

> What I haven't seen much of is discussion of protecting caches _as
> such_.  That is, given that we are going to cache, are there
> techniques that solve the dangers of a cache other than just
> preventing the cache from ever having the wrong data in the first
> place?=20=20

Here's an idea to contain the damage of a bad record by reducing the
amplification effect (attack one cache, compromise the network view
for thousands of clients):

If information enters the cache for the first time, you only use it a
fixed number of times before fetching it again from the network (say
10).  If the usage count is reached, you fetch the data from the
network (even if the TTL has not yet expired).  If it is still the
same, you double the counter.  If it is different, you fail back to
the initial value.

This will cause additional DNS traffic for those who publish unstable
data.  It is also reasonable to disable it during the cache warm-up
phase, and to keep records past their TTL (to avoid the cold start;
this makes sense for DNSSEC as well, were you often can avoid
cryptographic operations if the freshly fetched RRSIG matches the
stored one).

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=DFe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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>    I agree with you that there is a difference.   The problem
>    of course is that you often don't know that a ALG is also
>    installed in the NAT box.

If your (DHCP-derived) DNS server settings point at your router, it has an 
ALG in it.

Ray


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From owner-namedroppers@ops.ietf.org  Fri Aug 29 00:27:00 2008
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From: bert hubert <bert.hubert@netherlabs.nl>
To: Nicholas Weaver <nweaver@ICSI.Berkeley.EDU>
Cc: Namedroppers <namedroppers@ops.ietf.org>
Subject: Re: Stupid questions on stub resolvers...
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On Thu, Aug 28, 2008 at 08:31:25AM -0700, Nicholas Weaver wrote:
> Do people know of any stub resolvers which cache beyond the direct  
> answer when asking a recursive resolver?

Very little is known (at least, here) about the behaviour of the many
different stub resolvers.

Some applications (browsers) bring their own dedicated stub resolver, in
other cases the "stub resolver" is actually a repeater in a domestic router
or modem.

I suspect Microsoft Exchange to also have a built-in stub given its
unorthodox DNS behaviour at times.

This next to the stubs in phones, and the zoo of operating system versions.

More study might be in order. 

> EG, if the recursive resolver when asked "www.foo.com", also returns  
> an additional record "advertisements.foo.com A 12.34.56.78", will any  
> known stub resolvers cache that additional value?

I expect this behaviour to be very rare. CNAME chain following is about
where most stub resolvers end, in my expectaction.

	Bert

-- 
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From owner-namedroppers@ops.ietf.org  Fri Aug 29 00:51:36 2008
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Date: Fri, 29 Aug 2008 09:42:09 +0200
From: Stephane Bortzmeyer <bortzmeyer@nic.fr>
To: Paul Vixie <vixie@isc.org>
Cc: Jim Reid <jim@rfc1035.com>, Nicholas Weaver <nweaver@ICSI.Berkeley.EDU>,
	Namedroppers <namedroppers@ops.ietf.org>
Subject: Re: New Version Notification for draft-reid-dnsext-aleatoric-00
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On Thu, Aug 28, 2008 at 09:16:59PM +0000,
 Paul Vixie <vixie@isc.org> wrote 
 a message of 8 lines which said:

> 0x20 is a one-side upgrade (RDNS only).

Only if the aDNS preserves case which is currently NOT mandatory.

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 04:33:47 2008
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Subject: Re: Defending against the Kaminsky attack
Date: Fri, 29 Aug 2008 12:23:02 +0100
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----- Original Message ----- 
From: "Paul Vixie" <vixie@isc.org>
To: "George Barwood" <george@emsv.co.uk>
Cc: <namedroppers@ops.ietf.org>
Sent: Friday, August 22, 2008 9:16 PM
Subject: Re: Defending against the Kaminsky attack


> those are pattern-specific poison avoidances.  i'd much rather we focus
> on not accepting the bad response than on not letting its content hurt us.

[ I replied some days ago, but it seems to have got lost, possibly because I 
was at the beach so had to use an unsubscribed email address ]

I was not very definite on what checks I think are required, but the 
approach I am advocating ( with some encouragement from Nicholas Weaver via 
private email ), is completely general.

For definiteness, I'm here is the code I am using (see rough English 
translation below). The checking code is applied after parsing a DNS 
response, hopefully the meaning is self-evident. Records in each of the 
sections are initialised to be "Not ok", that is to be discarded.

  public void Check( int T, String Question, String Bailiwick )
  {
    if ( Answers.Length > 0 )
    {
      for (int i=0;i<Answers.Length;i+=1)
      {
        DnsRecord r = (DnsRecord)Answers[i];
        r.Ok = ( r.T == T || r.T == 5 ) && r.Name == Question;
      }
    }
    else // Referral
    {
      Hashtable GlueRequired = new Hashtable();
      for (int i=0;i<NameServers.Length;i+=1)
      {
        DnsRecord r = (DnsRecord)NameServers[i];
        r.Ok = r.T == 2 && r.Name.EndsWith( Bailiwick ) && r.Name != 
Bailiwick;
        if ( r.Ok )
        {
          String Rhs = (String)r.D.Data;
          if ( Rhs.EndsWith(r.Name) && Rhs != r.Name ) // Glue required
          {
            GlueRequired[Rhs] = Rhs;
          }
        }
      }
      for (int i=0;i<Additional.Length;i+=1)
      {
        DnsRecord r = (DnsRecord)Additional[i];
        r.Ok = r.T==1 && GlueRequired[r.Name] != null;
      }
    }
  }
}

This is in addition to "standard" checking of the Question section.

Rough translation into English:

If there are answers, ignore everything else.
Accept only answers where LHS matches the question.
If there are no answers, accept only proper referrals.
Glue is accepted only in one very specific case, that seems to be safe.

At least 3 questions arise:

(1) Is this code sufficient to successfully resolve names for properly 
configured domains?

(2) Does it prevent Kaminsky attacks?

(3) Is the performance penalty acceptable?

I believe the answer to all these questions is yes.



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From owner-namedroppers@ops.ietf.org  Fri Aug 29 05:23:49 2008
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On Aug 29, 2008, at 12:42 AM, Stephane Bortzmeyer wrote:

> On Thu, Aug 28, 2008 at 09:16:59PM +0000,
> Paul Vixie <vixie@isc.org> wrote
> a message of 8 lines which said:
>
>> 0x20 is a one-side upgrade (RDNS only).
>
> Only if the aDNS preserves case which is currently NOT mandatory.

This is why 0x20, IIRC, has "Duplicate on failure".

the aDNS in practice almost always preserves case, and duplication  
gives you a fallback position when you have insufficient entropy.



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From owner-namedroppers@ops.ietf.org  Fri Aug 29 06:10:23 2008
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From: "George Barwood" <george.barwood@blueyonder.co.uk>
To: <namedroppers@ops.ietf.org>
Subject: More 0x20 craziness
Date: Fri, 29 Aug 2008 13:59:57 +0100
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When sending a query to a root or 1st level server, it seems you can =
prepend a sufficiently long arbitrary label (say 80 Xs, or 10 random =
characters), giving as much entropy as you want either via 0x20, or just =
by simply checking the Question in the response.

It sounds crazy, but I have just tried it and it seems to work. Or maybe =
it is me that has gone crazy.

I'm not sure if there are any hidden assumptions here that might need to =
be standardised, or whether these random prefixes could cause any =
problems for the root / 1st level servers?

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<!DOCTYPE HTML PUBLIC "-//W3C//DTD HTML 4.0 Transitional//EN">
<HTML><HEAD>
<META http-equiv=3DContent-Type content=3D"text/html; =
charset=3Diso-8859-1">
<META content=3D"MSHTML 6.00.6000.16705" name=3DGENERATOR>
<STYLE></STYLE>
</HEAD>
<BODY bgColor=3D#ffffff>
<DIV><FONT face=3DArial size=3D2>When sending a query to a root or 1st =
level server,=20
it seems you&nbsp;can&nbsp;prepend a sufficiently long arbitrary label =
(say 80=20
Xs, or 10 random characters), giving as much entropy as you want either =
via=20
0x20, or just by simply checking the Question in the =
response.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>It sounds crazy, but I have just tried =
it and it=20
seems to work. Or maybe it is me that has gone crazy.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>I'm not sure if there are&nbsp;any =
hidden=20
assumptions here that might need to be standardised, or whether these=20
random&nbsp;prefixes&nbsp;could cause any problems for the root / 1st =
level=20
servers?</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV></BODY></HTML>

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 06:38:34 2008
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On Fri, Aug 29, 2008 at 01:59:57PM +0100,
 George Barwood <george.barwood@blueyonder.co.uk> wrote 
 a message of 61 lines which said:

> It sounds crazy, 

Isn't it simply XQID?

http://www.jhsoft.com/dns-xqid.htm

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 06:58:48 2008
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Subject: Re: More 0x20 craziness
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> Isn't it simply XQID?

But it doesn't need any change in the servers, so can work today.

But I'm now looking at what may prove to be a mirage, but appears to be 
wonderful, a miracle.

(1) Find the correct name server(s) (if not in cache). During this phase, 
prepend a random label to the question, so that there is no lack of entropy, 
rendering spoofing impossible. Only relies on authoritative servers copying 
Question back, not 0x20. No repetition needed.

(2) Submit the client query to the name server(s). Duing this phase ignore
Authority and Additional sections, only accept Answers where LHS matches 
question.
Repeat to gain more entropy if desired.

I haven't tried this yet, so may be horribly mistaken!








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From owner-namedroppers@ops.ietf.org  Fri Aug 29 07:04:38 2008
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From: Stephane Bortzmeyer <bortzmeyer@nic.fr>
To: George Barwood <george.barwood@blueyonder.co.uk>
Cc: namedroppers@ops.ietf.org
Subject: Re: More 0x20 craziness
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On Fri, Aug 29, 2008 at 01:59:57PM +0100,
 George Barwood <george.barwood@blueyonder.co.uk> wrote 
 a message of 61 lines which said:

> When sending a query to a root or 1st level server,

OK, I understand better now your idea and how it is different from
XQID. But, then, it seems it will work only with delegation-only
zones, no? It is not the case of every TLD...

This works, you get the right referral:

% dig @a-dns.pl A aNTIForgeRYstuFf-www.google.pl            

; <<>> DiG 9.5.0-P2 <<>> @a-dns.pl A aNTIForgeRYstuFf-www.google.pl
; (1 server found)
;; global options:  printcmd
;; Got answer:
;; ->>HEADER<<- opcode: QUERY, status: NOERROR, id: 18522
;; flags: qr rd; QUERY: 1, ANSWER: 0, AUTHORITY: 2, ADDITIONAL: 0
;; WARNING: recursion requested but not available

;; QUESTION SECTION:
;aNTIForgeRYstuFf-www.google.pl.        IN      A

;; AUTHORITY SECTION:
google.pl.              86400   IN      NS      ns1.google.com.
google.pl.              86400   IN      NS      ns2.google.com.

But this does not:

% dig @a-dns.pl A ANTiForgeRYstuFF-b-dns.pl

; <<>> DiG 9.5.0-P2 <<>> @a-dns.pl A ANTiForgeRYstuFF-b-dns.pl
; (1 server found)
;; global options:  printcmd
;; Got answer:
;; ->>HEADER<<- opcode: QUERY, status: NXDOMAIN, id: 4023

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 07:26:00 2008
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From: Alex Bligh <alex@alex.org.uk>
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To: Stephane Bortzmeyer <bortzmeyer@nic.fr>,
 George Barwood <george.barwood@blueyonder.co.uk>
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--On 29 August 2008 15:54:40 +0200 Stephane Bortzmeyer <bortzmeyer@nic.fr> 
wrote:

> But this does not:
> % dig @a-dns.pl A ANTiForgeRYstuFF-b-dns.pl
>
> ; <<>> DiG 9.5.0-P2 <<>> @a-dns.pl A ANTiForgeRYstuFF-b-dns.pl
> ; (1 server found)
> ;; global options:  printcmd
> ;; Got answer:
> ;; ->>HEADER<<- opcode: QUERY, status: NXDOMAIN, id: 4023

As I read what George was suggesting, you've addressed that to the
wrong server, and the correct query would be:

$ dig @a.root-servers.net A ANTiForgeRYstuFF-b-dns.pl

; <<>> DiG 9.4.2-P1 <<>> @a.root-servers.net A ANTiForgeRYstuFF-b-dns.pl
; (1 server found)
;; global options:  printcmd
;; Got answer:
;; ->>HEADER<<- opcode: QUERY, status: NOERROR, id: 62848
;; flags: qr rd; QUERY: 1, ANSWER: 0, AUTHORITY: 7, ADDITIONAL: 9
;; WARNING: recursion requested but not available

;; QUESTION SECTION:
;ANTiForgeRYstuFF-b-dns.pl.	IN	A

;; AUTHORITY SECTION:
pl.			172800	IN	NS	B-DNS.pl.
pl.			172800	IN	NS	G-DNS.pl.
pl.			172800	IN	NS	E-DNS.pl.
pl.			172800	IN	NS	F-DNS.pl.
pl.			172800	IN	NS	H-DNS.pl.
pl.			172800	IN	NS	A-DNS.pl.
pl.			172800	IN	NS	D-DNS.pl.

;; ADDITIONAL SECTION:
A-DNS.pl.		172800	IN	A	195.187.245.44
B-DNS.pl.		172800	IN	A	80.50.50.10
D-DNS.pl.		172800	IN	A	213.172.174.70
E-DNS.pl.		172800	IN	A	213.218.118.26
F-DNS.pl.		172800	IN	A	217.17.46.189
F-DNS.pl.		172800	IN	AAAA	2001:1a68:0:10::189
G-DNS.pl.		172800	IN	A	149.156.1.6
G-DNS.pl.		172800	IN	AAAA	2001:6d8:0:1::a:6
H-DNS.pl.		172800	IN	A	194.0.1.2



Alex

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 07:26:59 2008
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On Fri, Aug 29, 2008 at 03:16:40PM +0100,
 Alex Bligh <alex@alex.org.uk> wrote 
 a message of 53 lines which said:

> As I read what George was suggesting, you've addressed that to the
> wrong server, and the correct query would be:
>
> $ dig @a.root-servers.net A ANTiForgeRYstuFF-b-dns.pl

No, I do not think I was wrong, George mentioned the root servers but
also the TLD servers.

I we limit his scheme to the root servers, it works *today* (the root
is delegation-only) but it is quite limited.

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Date: Fri, 29 Aug 2008 16:57:23 +0200
From: Mohsen Souissi <mohsen.souissi@nic.fr>
To: namedroppers@ops.ietf.org
Subject: Re: More 0x20 craziness
Message-ID: <20080829145723.GC79975@kerkenna.nic.fr>
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 On 29 Aug, Stephane Bortzmeyer wrote:
 | On Fri, Aug 29, 2008 at 03:16:40PM +0100,
 |  Alex Bligh <alex@alex.org.uk> wrote 
 |  a message of 53 lines which said:
 | 
 | > As I read what George was suggesting, you've addressed that to the
 | > wrong server, and the correct query would be:
 | >
 | > $ dig @a.root-servers.net A ANTiForgeRYstuFF-b-dns.pl
 | 
 | No, I do not think I was wrong, George mentioned the root servers but
 | also the TLD servers.
 | 
 | I we limit his scheme to the root servers, it works *today* (the root
 | is delegation-only) but it is quite limited.
                           ^^^^^^^^^^^^^^^^^^^

==> I suspect it is even much more limited than you think, unless I
have missed something...

While there are no changes on the servers side, I think it is not the
case for the stub resolver.

As a matter of fact, while it is straigthforward to manually prepend
some an extra string to the original QNAME and then submit the new
query to root/tld servers by using some special DNS client like "dig",
which entity would/should do such prepending for *real DNS traffic*
typically originated by applications:

- the stub resolver when being invoked by the application, and in that
  case it would forget about the QNAME, unless it sends two queries
  (one with prepending and a second one without prepending)?

- the recursive name server (rdns) queried by the stub resolver on
  behalf of the application behind it? And in that case, would the
  rdns store the original query and send it the second time after the
  prepended query?

So in both cases, I don't think it works *today as is* without hacking
either one of the entities above. 


Mohsen.

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 08:10:56 2008
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> But this does not:
> 
> % dig @a-dns.pl A ANTiForgeRYstuFF-b-dns.pl

What you want here is ANTiForgRYstuFF.b-dns.pl (dot, not hyphen).  That
allows you to determine whether b-dns.pl is a zone apex.  In this case it
isn't, so you get NXDOMAIN and you know the closest enclosing zone is "pl".
"foo.pl", on the other hand, is a zone apex and "dig @a-dns.pl A
alkjerf.foo.pl" does get you the proper delegation.

(I've been playing with the same idea for a few days; Paul Vixie
mentioned it here yesterday in the post "kaminsky resistance, section
by section".)

-- 
Evan Hunt -- evan_hunt@isc.org
Internet Systems Consortium, Inc.

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From: Andrew Sullivan <ajs@commandprompt.com>
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Subject: Re: More 0x20 craziness
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[no hat]

On Fri, Aug 29, 2008 at 01:59:57PM +0100, George Barwood wrote:

> When sending a query to a root or 1st level server, it seems you can
> prepend a sufficiently long arbitrary label (say 80 Xs, or 10 random
> characters), giving as much entropy as you want either via 0x20, or
> just by simply checking the Question in the response.

Well, that happens to work for your current cases.  But how can you
possibly know that without asking?

A

-- 
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http://www.commandprompt.com/

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Alex Bligh wrote:
> As I read what George was suggesting, you've addressed that to the
> wrong server, and the correct query would be:

This is essentially the same (if not identical) as Paul was talking about 
in his "Section by Section" e-mail from last night - adding a random 
prefix on the front of the QNAME during delegation chain resolution.

The hardest part is zone-cuts.  For example, if I've got:

$ORIGIN example.com
www     IN      NS      ns1.example.net

  and

$ORIGIN www.example.com
@       IN      A       192.168.1.1

- how do we identify those without doing every (final) query twice? 

Asking for <nonce>.www.example.com to the root and .com servers will give 
high entropy queries that get you the delegation chain as far as 
example.com's nameservers.  But if we then only ask those servers the 
original question we've got no additional entropy on the resulting 
referral.  So (as Paul said) you still have to ask for 
<nonce>.www.example.com, and then get the referral, and then finally get 
NXDOMAIN, and only then can you ask the original question.

That appears to mean twice as many queries to the real authoritative 
servers, for every QNAME, since it's perfectly possible for 
foo.example.com to have a different final delegation chain to 
www.example.com.

Ray

I also came up with this independently earlier this month, but only 
mentioned it to Roy and Wouter and didn't happen to mention it to Paul.

-- 
Ray Bellis, MA(Oxon)
Senior Researcher in Advanced Projects, Nominet
e: ray@nominet.org.uk, t: +44 1865 332211


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> > 0x20 is a one-side upgrade (RDNS only).
> 
> Only if the aDNS preserves case which is currently NOT mandatory.

since the draft allows for this situation and explains what to do about it,
and since i've implemented it and have run it successfully for six months,
and since unbound has implemented it and noone has reported trouble there,
i think it's safe to categorize this as "RDNS only".  i know there is text
in the draft asking that the standard for ADNS be changed to optimize for
dns-0x20, but the current proposal is to add "SHOULD preserve qname case"
not "MUST preserve qname case."

contrast this with PING, XQID, AL, or things which don't work at all until
changes are made to the ADNS side.

so, i'd like dns-0x20 and AL not to be mentioned in the same breath, please.

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From: Paul Vixie <vixie@isc.org>
To: "George Barwood" <george.barwood@blueyonder.co.uk>
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> From: "Paul Vixie" <vixie@isc.org>
> To: "George Barwood" <george@emsv.co.uk>
> Cc: <namedroppers@ops.ietf.org>
> ...
> Rough translation into English:
> 
> If there are answers, ignore everything else.
> Accept only answers where LHS matches the question.
> If there are no answers, accept only proper referrals.
> Glue is accepted only in one very specific case, that seems to be safe.
> 
> At least 3 questions arise:
> 
> (1) Is this code sufficient to successfully resolve names for properly 
> configured domains?

no.  because you don't know whether you have an answer until you've looked
at the authority section.  answers are cacheable facts, not rrsets per se,
and the enumeration is at least:

	authoritative answer, no data for requested type
	nonauthoritative answer, no data for requested type
	name does not exist, not even as an empty nonterminal
	delegation
	server failure

note that the AA bit doesn't help much.  it might be set in an answer from
some zone who also sent you a delegation to a subzone, in which case the
answer isn't authoritative no matter what the AA bit tells you.

in any case, 'if there are answers, ignore all else' is bad out the gate.

> (2) Does it prevent Kaminsky attacks?
> 
> (3) Is the performance penalty acceptable?
> 
> I believe the answer to all these questions is yes.

did you read the proposal i sent out yesterday ("...section by section") ?

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> When sending a query to a root or 1st level server, it seems you can =
> prepend a sufficiently long arbitrary label (say 80 Xs, or 10 random =
> characters), giving as much entropy as you want either via 0x20, or just =
> by simply checking the Question in the response.
> 
> It sounds crazy, but I have just tried it and it seems to work. Or maybe =
> it is me that has gone crazy.
> 
> I'm not sure if there are any hidden assumptions here that might need to =
> be standardised, or whether these random prefixes could cause any =
> problems for the root / 1st level servers?

aside from the fact that some names are really in those zones and so no rule
of the form "if it's a top level or root zone query, behave as follows" can
scale, this duplicate some elements of a proposal i sent here yesterday (which
lacks this scaling limit) entitled "kaminsky resistance, section by section."

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> - how do we identify those without doing every (final) query twice? 

we don't.  that's the cost.

> That appears to mean twice as many queries to the real authoritative
> servers, for every QNAME, since it's perfectly possible for
> foo.example.com to have a different final delegation chain to
> www.example.com.

once per new QNAME per RDNS per TTL.  this is a lower number than you'd think.

> I also came up with this independently earlier this month, but only 
> mentioned it to Roy and Wouter and didn't happen to mention it to Paul.

i've also seen it mentioned in various non-mailing-list discussions all
year during the kaminsky exercises, but it could never overcome its
cost:benefit analysis until evan hunt mentioned it yesterday while i was
trying to figure out once again a way to delete contested NS RRsets from
the cache without immediately getting them poisoned by an attacker who
knew i'd be going uphill to refresh them.

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 09:43:58 2008
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--On 29 August 2008 16:10:39 +0000 Paul Vixie <vixie@isc.org> wrote:

>> - how do we identify those without doing every (final) query twice?
>
> we don't.  that's the cost.
>
>> That appears to mean twice as many queries to the real authoritative
>> servers, for every QNAME, since it's perfectly possible for
>> foo.example.com to have a different final delegation chain to
>> www.example.com.
>
> once per new QNAME per RDNS per TTL.  this is a lower number than you'd
> think.

If combined with 0x20, could one only make the additional query if
(i) the original qname's case was not preserved or (ii) the qname
did not itself contain sufficient entropy (e.g. ".", "com." etc.)?

Alex

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* Paul Vixie:

> since the draft allows for this situation and explains what to do about i=
t,
> and since i've implemented it and have run it successfully for six months,

Your setup is probably not representative (is it mail only?) because
it failed to detect initial breakage which other parties have observed
subsequently.

> and since unbound has implemented it and noone has reported trouble there,

<https://lists.dns-oarc.net/pipermail/dns-operations/2008-August/003183.htm=
l>

> i think it's safe to categorize this as "RDNS only".

I suppose that, as far as DNS changes go, 0x20 is relatively
risk-free.  But it's still a protocol change that affects responders
as well.

(I would prefer if the authors answered my previous question about
potential BCP 79 disclosures, though.)

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=DFe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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> >> - how do we identify those without doing every (final) query twice?
> >
> > we don't.  that's the cost.
> >
> >> That appears to mean twice as many queries to the real authoritative
> >> servers, for every QNAME, since it's perfectly possible for
> >> foo.example.com to have a different final delegation chain to
> >> www.example.com.
> >
> > once per new QNAME per RDNS per TTL.  this is a lower number than you'd
> > think.
> 
> If combined with 0x20, could one only make the additional query if
> (i) the original qname's case was not preserved or (ii) the qname
> did not itself contain sufficient entropy (e.g. ".", "com." etc.)?
> 
> Alex

i love the sound of that, except, there isn't "an" additional query in the
sense of "the one at the end that turns out to be one too many, that we'd
like to avoid".  you literally don't know which one is going to be the one
you'd be trying to avoid, until after you've received an answer to it.

however, if you changed this proposal to say "if there enough 0x20 bits
and if the servers all echo them properly, then it's not nec'y to fully
discover the NS RRset chain", then we could get a little further before
logjamming on two other issues.

issue the first is, the goal of this part of the proposal is to make it
possible to be very draconian in the NS RRset replacement strategy, and
i'm pretty sure that the number of bits i'd want to be protected by is
in the 64-or-so range when i'm about to make a predictable refill query.

issue the second is, one never knows if there's a UDP port derandomizer
somewhere in the path between an RDNS and an ADNS, so the number of 0x20
bits needed for full confidence is really 48 or so, and that's a very
long qname indeed.

great thought though.  you had me hoping there for a minute.

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From: Tony Finch <dot@dotat.at>
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On Thu, 28 Aug 2008, Paul Vixie wrote:

> for any given q-tuple where we have no specifically associated knowledge
> of its delegation chain, we can first ask for <randomstring>.<qname> and
> iterate downward along the returned NS RRsets until we receive one that
> isn't a delegation (indicating that "randomstring" matches a wildcard,
> or until we receive an NXDOMAIN.  since there's no way to be sure that
> www.<domain> and ftp.<domain> aren't zone apexes, we'll have to ask for
> <random>.www.<domain> and <random>.ftp.<domain> separately, even though
> we'll normally just learn that only <domain> has an NS RRset.  this
> extra cost allows us to commit to a draconian NS RRset replacement
> strategy: if a response contains an NS RRset which attempts to change
> the cache, then simply ignore the new one and delete the cached one, and
> restart iteration.

Doesn't that make it easy for an attacker to force you to spend all your
time rediscovering the victim domain's NS RRset so that you are never able
to resolve any victim names?

Tony.
-- 
f.anthony.n.finch  <dot@dotat.at>  http://dotat.at/
MALIN HEBRIDES BAILEY: SOUTHWESTERLY 5 OR 6,OCCASIONALLY 7 AT FIRST. MODERATE
OR ROUGH, OCCASIONALLY VERY ROUGH. RAIN OR DRIZZLE, FOG PATCHES IN MALIN,
SHOWERS IN BAILEY LATER. MODERATE OR GOOD, OCCASIONALLY VERY POOR IN MALIN.

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> > since the draft allows for this situation and explains what to do about it,
> > and since i've implemented it and have run it successfully for six months,
> 
> Your setup is probably not representative (is it mail only?) because
> it failed to detect initial breakage which other parties have observed
> subsequently.

it failed because i had a bug in my syslog() library call arguments and i
literally didn't know that it wasn't universally working.  i quickly fixed
that and found l.google.com and other nameservers, and the second 0x20 draft 
explained how to get confidence in the presence of a non-copying ADNS.  all
of this is in the record, and it does not invalidate the dns-0x20 approach.

and for the record my setup is far from mail-only.

> I suppose that, as far as DNS changes go, 0x20 is relatively risk-free.
> But it's still a protocol change that affects responders as well.

if it works today and will work whether or not any given ADNS is changed,
and if the proposed protocol change is a new SHOULD rather than a new MUST,
then i really think it's fair to categorize it as "RDNS only" when being
compared to other approaches that don't work at all until some/most/all
ADNS are changed.

> (I would prefer if the authors answered my previous question about
> potential BCP 79 disclosures, though.)

ISC holds no patents today and has never applied for a patent.  if we were
to apply for a patent some day and if it was granted, then our corporate
bylaws would mandate that the patent be universally available on an
unrestricted royalty free basis with no attribution requirements, similar
to the BSD license on our software.

david dagon was acting as an ISC no-fee consultant when he came up with the
idea of dns-0x20, and i was acting as an ISC employee when i wrote up the
draft and did the initial pilot implementation.

i hope this clarifies the BCP 79 status of dns-0x20.

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 10:32:51 2008
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> Doesn't that make it easy for an attacker to force you to spend all your
> time rediscovering the victim domain's NS RRset so that you are never able
> to resolve any victim names?

"easy" is in the eye of the beholder.  if noone is derandomizing your UDP
port numbers then it will take an average of ten hours at multi-hundred-mbit
to get you to do this one time.  and that's assuming you don't have good 0x20
connectivity, or a private invitation-only VPN that RDNS and ADNS are part of
but which attackers are mostly not, or TSIG, or TKEY, or PING, or DNSSEC.

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* Paul Vixie:

>> > since the draft allows for this situation and explains what to do abou=
t it,
>> > and since i've implemented it and have run it successfully for six mon=
ths,
>>=20
>> Your setup is probably not representative (is it mail only?) because
>> it failed to detect initial breakage which other parties have observed
>> subsequently.
>
> it failed because i had a bug in my syslog() library call arguments and i
> literally didn't know that it wasn't universally working.  i quickly fixed
> that and found l.google.com and other nameservers,

Ah, okay.  Thanks.

>> I suppose that, as far as DNS changes go, 0x20 is relatively risk-free.
>> But it's still a protocol change that affects responders as well.
>
> if it works today and will work whether or not any given ADNS is changed,

I don't think your detection logic handles the
NXDOMAIN-for-upper-case-but-echo-with-correct-echo case, but this one
is violating the RFC and is terminally broken anyway (potential DoS
through client query) and it should not be held against 0x20.

If we can't label 0x20 as a protocol change for procedural reasons,
I'm fine with that.

> i hope this clarifies the BCP 79 status of dns-0x20.

Yes, thank you very much.

--=20
Florian Weimer                <fweimer@bfk.de>
BFK edv-consulting GmbH       http://www.bfk.de/
Kriegsstra=DFe 100              tel: +49-721-96201-1
D-76133 Karlsruhe             fax: +49-721-96201-99

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From: Alex Bligh <alex@alex.org.uk>
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To: Paul Vixie <vixie@isc.org>
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 Alex Bligh <alex@alex.org.uk>
Subject: Re: More 0x20 craziness
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--On 29 August 2008 16:54:51 +0000 Paul Vixie <vixie@isc.org> wrote:

> i love the sound of that, except, there isn't "an" additional query in the
> sense of "the one at the end that turns out to be one too many, that we'd
> like to avoid".  you literally don't know which one is going to be the one
> you'd be trying to avoid, until after you've received an answer to it.

I need to think a bit more about that. I think a query by query illustration
of how the "section by section" approach works would help illustrate it
to people in general (not just me).

> issue the first is, the goal of this part of the proposal is to make it
> possible to be very draconian in the NS RRset replacement strategy, and
> i'm pretty sure that the number of bits i'd want to be protected by is
> in the 64-or-so range when i'm about to make a predictable refill query.
>
> issue the second is, one never knows if there's a UDP port derandomizer
> somewhere in the path between an RDNS and an ADNS, so the number of 0x20
> bits needed for full confidence is really 48 or so, and that's a very
> long qname indeed.

Is it a reasonable assumption that if "the internet" (perhaps signaled
by a couple of test probes) is not behind a port derandomiser, then
no nameserver is? IE is discovery that an RDNS is "behind" a derandomiser
(NAT / ALG etc.) sufficient to use as a heuristic for needing more
entropy in the qname (under 0x20 or some other proposal), or do we
also need to consider the case where any arbitrary ADNS might have
a derandomiser in front of it? I am thinking that if we could put
in the category of "if you run an ADNS like this you deserve to get
your domains spoofed more easily", then an RDNS which could detect
whether it is behind a NAT through queries to a couple of servers
that happened to support a suitable extension could by extension apply
(or not apply) that to all servers, and hence require more bits of
entropy.

A possible nit with approaches that rely on prepending data to
the qname is that they risk shortening the maximum 'true' qname
length. I think in the real world the heaviest user here is NSEC3
(no comments about DNSSEC and 'real world' in the same sentence
please) and one presumes that this isn't a problem.

Alex

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 11:19:45 2008
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Subject: Re: More 0x20 craziness
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I have now tried it out, and there seems to be a problem in some cases.

The akamaiedge.net Bailwick returns Name Error (3) for

<nonce>.E120.G.akamaiedge.net

with a SOA record ( and no name servers / referral ).

However in stage 2, it generates a referral for the question 
E120.G.akamaiedge.net

[ Client query was www.paypalobjects.com ]

It still seems to be a good trick for queries to root and TLD servers, but I 
still cannot see any way of getting high security for akamaiedge.net ( 
although of course 0x20 helps a bit ).



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Paul Vixie wrote on 08/29/2008 06:10:39 PM:

> Ray Bellis wrote on 08/29/2008 05:09:28 PM:
>
> > I also came up with this independently earlier this month, but only 
> > mentioned it to Roy and Wouter and didn't happen to mention it to 
Paul.
> 
> i've also seen it mentioned in various non-mailing-list discussions all
> year during the kaminsky exercises, but it could never overcome its
> cost:benefit analysis until evan hunt mentioned it yesterday while i was
> trying to figure out once again a way to delete contested NS RRsets from
> the cache without immediately getting them poisoned by an attacker who
> knew i'd be going uphill to refresh them.

Since I'm mentioned here, I'll respond.

Ray Bellis mentioned this idea to me on the 10th of August. I subsequently 
discussed it with Wouter Wijngaards as a possible scenario to add entropy 
during resolution of the delegation chain (for implementation in Unbound). 
I've not seen it mentioned before elsewhere. 

This is roughly what was discussed at the time:

During resolution, prepend a label with a nonce to the query. The query 
would look like <nonce>.www.example.com. Each request has a unique nonce, 
a nonce is never re-used.

This continues until an authoritative answer is received (either NXDOMAIN, 
wildcard, CNAME, DNAME, anything that either terminates or restarts the 
resolution process). That authoritative answer comes most likely from a 
server that is authoritative for the www.example.com domain. (most likely, 
since in theory, the <nonce>.www.example.com name could be delegated from 
the www.example.com domain, which is most unlikely, as that would suggest 
delegation point wildcard NS RRSets).

Anyway, we now have an address of a nameserver that is authoritative for 
www.example.com.
We could send it a priming query for the authoritative nameservers (Wouter 
Wijngaards idea).
In any case, we can now send it a query for www.example.com.

Regards

Roy

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 12:42:43 2008
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Date: Fri, 29 Aug 2008 15:31:03 -0400
From: Andrew Sullivan <ajs@commandprompt.com>
To: namedroppers@ops.ietf.org
Subject: Possible materials for meeting in Minneapolis?
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Dear colleagues,

The scheduling period for requesting a WG meeting in Minneapolis is
now open.  Given the current amount of activity going on, it is
possible that we will have material to discuss at such a meeting.  It
would be nice, however, if the Chairs could be confident there will be
actual Internet Drafts available for working group consideration.
Therefore, if you have or are working on a draft that you plan to ask
the WG to adopt, it would be good to hear about that now (while we
think about whether we need to schedule a session). 


Thanks,
Andrew (for the Chairs)


-- 
Andrew Sullivan
ajs@commandprompt.com
+1 503 667 4564 x104
http://www.commandprompt.com/

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Date: Fri, 29 Aug 2008 12:36:21 -0700
To: Andrew Sullivan <ajs@commandprompt.com>, namedroppers@ops.ietf.org
From: Paul Hoffman <paul.hoffman@vpnc.org>
Subject: Re: Protecting caches?
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At 1:08 PM -0400 8/27/08, Andrew Sullivan wrote:
>What I haven't seen much of is discussion of protecting caches _as
>such_.  That is, given that we are going to cache, are there
>techniques that solve the dangers of a cache other than just
>preventing the cache from ever having the wrong data in the first
>place?

What I have not seen, even post-Kaminsky, is a good discussion of 
what we put into a cache. For example, I am still befuddled about why 
part of the Kaminsky attack works. If I have a record in my cache 
with days left on the TTL, why should an attacker be able to change 
that record with bad information when I'm asking about a different 
record? The advantage of this ("we gave too long of a TTL and now 
need to move the IP address quickly") seems to be heavily outweighed 
by the ease of the attack.

--Paul Hoffman, Director
--VPN Consortium

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> > i love the sound of that, except, there isn't "an" additional query in the
> > sense of "the one at the end that turns out to be one too many, that we'd
> > like to avoid".  you literally don't know which one is going to be the one
> > you'd be trying to avoid, until after you've received an answer to it.
> 
> I need to think a bit more about that. I think a query by query
> illustration of how the "section by section" approach works would help
> illustrate it to people in general (not just me).

you're right of course.

> > issue the first is, the goal of this part of the proposal is to make it
> > possible to be very draconian in the NS RRset replacement strategy, and
> > i'm pretty sure that the number of bits i'd want to be protected by is
> > in the 64-or-so range when i'm about to make a predictable refill query.
> >
> > issue the second is, one never knows if there's a UDP port derandomizer
> > somewhere in the path between an RDNS and an ADNS, so the number of 0x20
> > bits needed for full confidence is really 48 or so, and that's a very
> > long qname indeed.
> 
> Is it a reasonable assumption that if "the internet" (perhaps signaled by
> a couple of test probes) is not behind a port derandomiser, then no
> nameserver is? IE is discovery that an RDNS is "behind" a derandomiser
> (NAT / ALG etc.) sufficient to use as a heuristic for needing more
> entropy in the qname (under 0x20 or some other proposal), ...

i'm saying no, because the probes can become a new vulnerability (to either
attacks, or implementation errors, or new kinds of middleboxes), and because
topology and topography can change.  and that's not counting the possibility
that an RDNS may be in a multipath topology where some packets get their UDP
port numbers derandomized and some do not.  there's too much variability, now
and in the future, for me to get comfortable with modality of this kind.  i'd
be a lot more comfortable if we came up with something we "just always do".

> A possible nit with approaches that rely on prepending data to the qname
> is that they risk shortening the maximum 'true' qname length. I think in
> the real world the heaviest user here is NSEC3 (no comments about DNSSEC
> and 'real world' in the same sentence please) and one presumes that this
> isn't a problem.
> 
> Alex

indeed, we're talking about burning some qname length.  however, i'm only
asking for 64 bits, which using base32 is eleven ASCII characters, which is
not a lot to take out of a 256-character quota.

---

note that many "nameservers" just don't answer some of the queries i'm saying
we should send to protect the authority section.  the NS's for www.cnn.com
just time out on "dig @dmtns01.turner.com. kjhsdfkjhsdf.www.cnn.com in a".
this is clearly not a real name server, it's a dns middlebox of some kind,
one of many that does the wrong thing.  (i don't mind somebody who doesn't
answer NS queries since these are always diagnostic in nature, but someone
who won't send a delegation unless they recognize the qname is just evil.)
((thanks to dan kaminsky's blog for pointing out the CNN example, and to
robert edmonds who shared it with me.))

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Subject: Re: nonce label prefix (was Re: More 0x20 craziness)
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> ...
> We could send it a priming query for the authoritative nameservers (Wouter 
> Wijngaards idea).
> ...

root name servers have to answer priming queries.
noone else has to, and many do not.

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 13:01:57 2008
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From:	 JINMEI Tatuya / =?ISO-2022-JP?B?GyRCP0BMQEMjOkgbKEI=?=
 <Jinmei_Tatuya@isc.org>
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Subject: Re: nonce label prefix (was Re: More 0x20 craziness)
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At Fri, 29 Aug 2008 20:17:29 +0200,
"Roy Arends" <roy@nominet.org.uk> wrote:

> During resolution, prepend a label with a nonce to the query. The query 
> would look like <nonce>.www.example.com. Each request has a unique nonce, 
> a nonce is never re-used.
> 
> This continues until an authoritative answer is received (either NXDOMAIN, 
> wildcard, CNAME, DNAME, anything that either terminates or restarts the 
> resolution process). That authoritative answer comes most likely from a 
> server that is authoritative for the www.example.com domain. (most likely, 
> since in theory, the <nonce>.www.example.com name could be delegated from 
> the www.example.com domain, which is most unlikely, as that would suggest 
> delegation point wildcard NS RRSets).
> 
> Anyway, we now have an address of a nameserver that is authoritative for 
> www.example.com.
> We could send it a priming query for the authoritative nameservers (Wouter 
> Wijngaards idea).
> In any case, we can now send it a query for www.example.com.

One thing I've puzzled about regarding this type of approach is its
cost-benefit tradeoff.  If we can only use it in identifying
intermediate NSes, I thought our 'best current practice' (i.e.,
randomized QID + source port (+ perhaps source IP address (+ perhaps
'traditional' 0x20))) already provided reasonable security.  We could
also use this to confirm possible change of already cached NS as
seemingly indicated in this thread, but for that purpose we can
actually simply fetch the authoritative NS RRset directly; then the
trust ranking concept of RFC2181 will protect us from further attacks.

Of course, the <nonce> or <random> makes the transaction even securer,
so if we can get it free, that would be wonderful; but it actually
comes with a cost, including more queries that are redundant
otherwise, handling miscellaneous corner cases or non compliant
authoritative servers, run-time cost including getting additional
entropy, and of course implementation cost (which is probably minor,
though).

So far, the tradeoff is not so obvious to me (indeed, it seems to me
the known benefit isn't worth the cost), but as no one else seems to
have the same doubt, am I missing something fundamental, or does the
benefit so obviously outweigh the cost for others?

---
JINMEI, Tatuya
Internet Systems Consortium, Inc.

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 13:02:12 2008
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--On 29 August 2008 19:41:57 +0000 Paul Vixie <vixie@isc.org> wrote:

> note that many "nameservers" just don't answer some of the queries i'm
> saying we should send to protect the authority section.  the NS's for
> www.cnn.com just time out on "dig @dmtns01.turner.com.
> kjhsdfkjhsdf.www.cnn.com in a". this is clearly not a real name server,
> it's a dns middlebox of some kind, one of many that does the wrong thing.
> (i don't mind somebody who doesn't answer NS queries since these are
> always diagnostic in nature, but someone who won't send a delegation
> unless they recognize the qname is just evil.) ((thanks to dan kaminsky's
> blog for pointing out the CNN example, and to robert edmonds who shared
> it with me.))

Well, I think breaking resolution for ADNS (or more accurately middlebox
infested ADNS) which are clearly and irrefutably non-compliant is an
acceptable price given vendors have now some time to fix it, assuming
the population isn't that large - after all port randomisation broke
many dubious firewall configs and was deemed acceptable, and I suspect
the total number of broken DNS middleboxen is far smaller than this.
I'm sure cnn.com have a vested interest in making sure cnn.com continues
to resolve, and far more ability to make sure it does than your
average Joe firewall user.

Alex

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if dns-0x20 has been adopted, then i'd like to get reviews and comments
so i can rev the draft before minneapolis.

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In-Reply-To: Your message of "Fri, 29 Aug 2008 12:36:21 MST."
             <p06240806c4ddfea3476c@[10.20.30.152]> 
References: <20080827170822.GH18946@commandprompt.com>  <p06240806c4ddfea3476c@[10.20.30.152]> 
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> What I have not seen, even post-Kaminsky, is a good discussion of 
> what we put into a cache. For example, I am still befuddled about why 
> part of the Kaminsky attack works. If I have a record in my cache 
> with days left on the TTL, why should an attacker be able to change 
> that record with bad information when I'm asking about a different 
> record? The advantage of this ("we gave too long of a TTL and now 
> need to move the IP address quickly") seems to be heavily outweighed 
> by the ease of the attack.
> 
> --Paul Hoffman, Director
> --VPN Consortium

RFC 2181 codified a credibility ranking system which controlled some
aspects of cache replacement.  it's possible that it should have said
more, gone further.  however, it's ultimately desireable that a long
TTL not lock out same-credibility replacement data.  TTL is about 
expiry not replacement.

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 13:28:14 2008
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References: <20080827170822.GH18946@commandprompt.com> 
 <p06240806c4ddfea3476c@[10.20.30.152]> <27375.1220039713@nsa.vix.com>
Date: Fri, 29 Aug 2008 13:17:58 -0700
To: Paul Vixie <vixie@isc.org>
From: Paul Hoffman <paul.hoffman@vpnc.org>
Subject: Re: Protecting caches?
Cc: Andrew Sullivan <ajs@commandprompt.com>, namedroppers@ops.ietf.org
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At 7:55 PM +0000 8/29/08, Paul Vixie wrote:
>  > What I have not seen, even post-Kaminsky, is a good discussion of
>>  what we put into a cache. For example, I am still befuddled about why
>>  part of the Kaminsky attack works. If I have a record in my cache
>>  with days left on the TTL, why should an attacker be able to change
>>  that record with bad information when I'm asking about a different
>>  record? The advantage of this ("we gave too long of a TTL and now
>>  need to move the IP address quickly") seems to be heavily outweighed
>>  by the ease of the attack.
>>
>>  --Paul Hoffman, Director
>>  --VPN Consortium
>
>RFC 2181 codified a credibility ranking system which controlled some
>aspects of cache replacement.

Right.

>it's possible that it should have said
>more, gone further.

Or that it should be reconsidered in the current light. A small 
modification to the text might go a long way. For example, it says:

    Unauthenticated RRs received and cached from the least trustworthy of
    those groupings, that is data from the additional data section, and
    data from the authority section of a non-authoritative answer, should
    not be cached in such a way that they would ever be returned as
    answers to a received query.  They may be returned as additional
    information where appropriate.  Ignoring this would allow the
    trustworthiness of relatively untrustworthy data to be increased
    without cause or excuse.

Adding "or glue from a primary zone" to the list in the first 
sentence would eliminate the effects of the Kaminsky attack, would it 
not?

>however, it's ultimately desireable that a long
>TTL not lock out same-credibility replacement data.  TTL is about
>expiry not replacement.

That is the crux of the question. It sounds like you disagree with my 
assessment that the disadvantage of this policy (the Kaminsky attack) 
is stronger than the advantage (allowing replacement before expiry, 
even if the replacement is from an attacker).

--Paul Hoffman, Director
--VPN Consortium

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 13:35:08 2008
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> Adding "or glue from a primary zone" to the list in the first sentence
> would eliminate the effects of the Kaminsky attack, would it not?

for replacement, but not insertion, yes.

> >however, it's ultimately desireable that a long TTL not lock out
> >same-credibility replacement data.  TTL is about expiry not replacement.
> 
> That is the crux of the question. It sounds like you disagree with my
> assessment that the disadvantage of this policy (the Kaminsky attack) is
> stronger than the advantage (allowing replacement before expiry, even if
> the replacement is from an attacker).

i know there are a lot of working configurations which depend on low latency
cache replacement and so have long ttl's.  we'd be breaking these.  i suspect
that there are more such currently working configurations than i know about.

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> but for that purpose we can actually simply fetch the authoritative
> NS RRset directly; then the trust ranking concept of RFC2181 will
> protect us from further attacks.

The problem as I saw it is that the real authoritative NS RRset (the one 
that's in the delegated zone) has to be fetched from an IP address which 
is learnt from DNS requests which are less credible (per RFC2181 rules).

Or, to put it another way, you're suggesting that we believe 5th tier 
information ("glue from a primary zone") to get 3rd tier information 
("authoritative data included in the answer section of an authoritative 
reply").

However, the Kaminksy attack pollutes the cache with spoofed 4th tier data 
("data from the authority section of an authoritative answer").
_
So, we've a known attack against tier 4, but we have to _really_ believe 
the tier 5 data before we can reliably obtain the real tier 3 data.

Ray


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At Fri, 29 Aug 2008 22:44:35 +0100,
Ray.Bellis@nominet.org.uk wrote:

> > but for that purpose we can actually simply fetch the authoritative
> > NS RRset directly; then the trust ranking concept of RFC2181 will
> > protect us from further attacks.
> 
> The problem as I saw it is that the real authoritative NS RRset (the one 
> that's in the delegated zone) has to be fetched from an IP address which 
> is learnt from DNS requests which are less credible (per RFC2181 rules).
> 
> Or, to put it another way, you're suggesting that we believe 5th tier 
> information ("glue from a primary zone") to get 3rd tier information 
> ("authoritative data included in the answer section of an authoritative 
> reply").

Right, but that part is established by "identifying intermediate NSes"
(quoting my previous message) and "I thought our 'best current
practice' (i.e., randomized QID + source port (+ perhaps source IP
address (+ perhaps 'traditional' 0x20))) already provided reasonable
security" (ditto).  Note that the available window for the attacker is
very limited (generally, just once per TTL) because we'd trigger the
confirmation query if we detect an update attempt with different
information.

Again, I understand the additional nonce makes this process even
securer.  My question is whether the benefit outweighs its cost.

---
JINMEI, Tatuya
Internet Systems Consortium, Inc.

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 15:44:13 2008
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Date: Fri, 29 Aug 2008 15:36:00 -0700
To: Paul Vixie <vixie@isc.org>
From: Paul Hoffman <paul.hoffman@vpnc.org>
Subject: Re: Protecting caches?
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At 8:26 PM +0000 8/29/08, Paul Vixie wrote:
>  > Adding "or glue from a primary zone" to the list in the first sentence
>>  would eliminate the effects of the Kaminsky attack, would it not?
>
>for replacement, but not insertion, yes.

Agree.

>  > >however, it's ultimately desireable that a long TTL not lock out
>>  >same-credibility replacement data.  TTL is about expiry not replacement.
>>
>>  That is the crux of the question. It sounds like you disagree with my
>>  assessment that the disadvantage of this policy (the Kaminsky attack) is
>>  stronger than the advantage (allowing replacement before expiry, even if
>>  the replacement is from an attacker).
>
>i know there are a lot of working configurations which depend on low latency
>cache replacement and so have long ttl's.  we'd be breaking these.  i suspect
>that there are more such currently working configurations than i know about.

Could you (or someone) describe these? What is their reason for a 
long TTL if they know there is going to be a replacement?

--Paul Hoffman, Director
--VPN Consortium

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From owner-namedroppers@ops.ietf.org  Fri Aug 29 16:00:26 2008
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> Well, I think breaking resolution for ADNS (or more accurately middlebox
> infested ADNS) which are clearly and irrefutably non-compliant is an
> acceptable price given vendors have now some time to fix it, assuming the
> population isn't that large - after all port randomisation broke many
> dubious firewall configs and was deemed acceptable, and I suspect the
> total number of broken DNS middleboxen is far smaller than this.  I'm
> sure cnn.com have a vested interest in making sure cnn.com continues to
> resolve, and far more ability to make sure it does than your average Joe
> firewall user.

i'm not sure how successful bind or unbound or nominum would be with a
patch that broke www.cnn.com, however.

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> So far, the tradeoff is not so obvious to me (indeed, it seems to me
> the known benefit isn't worth the cost), but as no one else seems to
> have the same doubt, am I missing something fundamental, or does the
> benefit so obviously outweigh the cost for others?
> 
> ---
> JINMEI, Tatuya
> Internet Systems Consortium, Inc.

i am also reconsidering these issues.

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	draft-andrews-dnsext-expire-XX

-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Sat Aug 30 01:10:37 2008
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I now agree that this whole idea ( of performing checks other than the 
standard Bailiwick check ) is a dead end. It just doesn't work, thanks to 
Wouter Winjgaards for pointing me to the case of  Peter Koch's 'phantom 
referral', so the only way forward is getting more entropy.

I believe there are 3 mechanisms that work.

(1) The 0x20 proposal.

(2) For Root and TLD queries, prepending a random nonce to the question.

(3) Repeating the query, and using a temporary data structure to "converge" 
the result.
Recently expired cache entries can be taken into account so that for TTL 
refresh operations, repetition is not required.

[ I am trying this, and so far it works very nicely at  50 bits of entropy, 
without random source port ]



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Subject: Re: Some Observations on Entropy Re: Some observations on dns-0x20
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References: <200808290117.m7T1HAWd037207@drugs.dv.isc.org> <72632.1219976772@nsa.vix.com>
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> agreed.  testing for this and responding to it adds complexity and doesn't
> nec'ily buy you anything if the ADNS you're querying is behind their own
> local NAT-based derandomizer.

The only circumstance I've thought of where that is true is where the attacker is behind that NAT device and is capable of spoofing packets.  This is surely a very rare position. 

MITM attacks are possible in most of those positions; e.g. ARP spoofing the gateway. It's up to the ADNS operator to ensure their network isn't braindead. Furthermore, I think ADNSs are rarely behind NAT devices.

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From owner-namedroppers@ops.ietf.org  Sat Aug 30 12:57:18 2008
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From: bert hubert <bert.hubert@netherlabs.nl>
To: Paul Hoffman <paul.hoffman@vpnc.org>
Cc: Andrew Sullivan <ajs@commandprompt.com>,
	namedroppers@ops.ietf.org
Subject: Re: Protecting caches?
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On Fri, Aug 29, 2008 at 12:36:21PM -0700, Paul Hoffman wrote:
> part of the Kaminsky attack works. If I have a record in my cache 
> with days left on the TTL, why should an attacker be able to change 
> that record with bad information when I'm asking about a different 
> record? The advantage of this ("we gave too long of a TTL and now 

Most programmers of servers used to act on the assumption that packets (and
by extension, questions) were expensive. An answer carrying 'free' data for
which the resolver considered it authoritative was more than welcome in this
respect.

Plus the oft quoted credibility rules of course.

I'm moving to having a switch that lets data with an unexpired TTL not be
overwritten by newer answers.

	Bert

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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From owner-namedroppers@ops.ietf.org  Sat Aug 30 13:42:06 2008
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Subject: dnscurve -- new or did I just miss this?
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http://dnscurve.org/

DNSCurve uses high-speed high-security elliptic-curve cryptography to 
drastically improve every dimension of DNS security:

     * Confidentiality: DNS requests and responses today are completely 
unencrypted and are broadcast to any attacker who cares to look. 
DNSCurve encrypts all DNS packets.
     * Integrity: DNS today uses "UDP source-port randomization" and 
"TXID randomization" to create some speed bumps for blind attackers, but 
patient attackers and sniffing attackers can easily forge DNS records. 
DNSCurve cryptographically authenticates all DNS responses, eliminating 
forged DNS packets.
     * Availability: DNS today has no protection against denial of 
service. A sniffing attacker can disable all of your DNS lookups by 
sending just a few forged packets per second. DNSCurve very quickly 
recognizes and discards forged packets, so attackers have much more 
trouble preventing DNS data from getting through. Protection is also 
needed for SMTP, HTTP, HTTPS, etc., but protecting DNS is the first step.

Despite its extremely high level of security, DNSCurve is very easy for 
software authors to implement, and very easy for administrators to deploy.

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PiBkbnNjdXJ2ZSAtLSBuZXcgb3IgZGlkIEkganVzdCBtaXNzIHRoaXM/CgpDcmVhdGVkIE9uOjEw
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From owner-namedroppers@ops.ietf.org  Sat Aug 30 15:48:03 2008
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Subject: Re: dnscurve -- new or did I just miss this?
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> Created On:10-Aug-2008 06:32:59 UTC
> Last Updated On:27-Aug-2008 13:17:39 UTC
> Registrant Name:Daniel J. Bernstein
> 
> > http://dnscurve.org/
> 
> I have read those pages and as I understand them djb proposes
> encrypting DNS communication (encapsulating it into TXT query
> and response) when it sees some special string in domain
> name ('uz5').
> 
> But since DNSCurve doesn't have trust anchors it does not protect
> you before you get this new special name (which is distributed
> by PODS).  I can even spoof DNSCurve nameserver and my *evil*
> DNS server can talk DNSCurve protocol.  Basicaly it's like
> self-signed certificates.
> 
> Or am I missing something?

>From my reading of it, the key is distributed in the domain name; one would need some secure (OOB) method to authenticate the domain names. One could have a trust anchor equivelant by only using pre-configured nameservers for certain domains, perhaps allowing parent nameservers to override it if they were quried using DNSCurve. If this were enabled at the root (<sarcasm>I'm sure that would not cause any load issues</sarcasm>), then no trust anchor would be needed for verification -- the root server names themselves could be used. 

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From owner-namedroppers@ops.ietf.org  Sat Aug 30 16:12:25 2008
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Date: Sun, 31 Aug 2008 07:25:23 +1000
To: namedroppers@ops.ietf.org
From: Edward Lewis <Ed.Lewis@neustar.biz>
Subject: Re: Zone Immortality
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At 14:28 +1000 8/21/08, Mark Andrews wrote:
>	* Outlaw loops.
>	* Don't reset the expire counter on refresh from peers only
>	  on transfer from peers.

I'd reset the expiry only after the successful transfer of an zone 
with an incremented serial number.  That would take care of loops.

>	* Use DNSSEC to make data go stale.

Don't do that.  Don't overload the meaning of the RRSIG temporal 
fields.  They are meant to protect the cryptography, not convey any 
meaning of the data.

At 1:00 -0400 8/21/08, Brian Dickson wrote:
>If a zone is transfered *from* a slave, the values for the TTLs should
>be modified downwards by the local EXPIRE timer. Only transfers from a
>zone master should have the original TTL values from the SOA used for timers.

The problem is distinguishing between a master and a slave.

At 14:52 +0900 8/21/08, Masataka Ohta wrote:
>A hidden assumption of 1034 is that such convergence will occur
>within a period much shorter than the expiration period.

Many assumptions of that era no longer are valid. ;)

>If not, you have an administrative problem a lot more serious
>than a small variation of expiraiton period.

Not necessarily.  There are applications of DNS on disjointed 
networks such as very remote places (which hardly exist anymore), 
sea-going vessels, inter-planetary applications.
-- 
-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-=-
Edward Lewis                                                +1-571-434-5468
NeuStar

Never confuse activity with progress.  Activity pays more.

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From owner-namedroppers@ops.ietf.org  Sat Aug 30 16:54:13 2008
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From: list-namedroppers@pwns.ms
To: namedroppers@ops.ietf.org
Subject: Re: dnscurve -- new or did I just miss this?
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References: <48B9AE7C.4070703@everydns.net> <e90946380808301452t7257f3f4tfd375c41f47fb560@mail.gmail.com> <20080830223839.GA15555@pwns.ms> <e90946380808301628t4b176172vea77dd4dcf148cda@mail.gmail.com>
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> But it has some interesting ideas.  I am not a crypto guy, so maybe I
> am wrong, but could we use that elliptic curve cryptography in place
> of RSA?

I think so. RFC4034 defines algorithim number 4 for elliptic curves, but I don't see any definition for it's usage.

Implementors and cryptographers tend to be unfamiliar with elliptic curves, which is mildly scary. Elliptic curves are well supported by common crypto libraries, but still much less so than RSA - I doubt this would be a problem, though. RSA works, so there is little motivation to moving to elliptic curves.

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From: "George Barwood" <george.barwood@blueyonder.co.uk>
To: <namedroppers@ops.ietf.org>
Subject: Repeat queries to non-deterministic servers
Date: Sun, 31 Aug 2008 08:35:58 +0100
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When sending a repeat request ( to increase entropy ), some name servers =
give different replies on each request.

Has anyone considered the best way to handle this?=20

My current heuristic is to count

Total =3D Total number of distinct records seen.
ConfTotal =3D Total number of distinct records confirmed ( total entropy =
above threshold of 50 bits ).

and to stop when

Total > 0 and Total =3D ConfTotal // the normal case for deterministic =
servers
or ConfTotal > 30
or in any case after 20 queries.

An example is found when resolving the host E120.G.AKAMAIEDGE.NET

Using the heuristic above, this stops with Total=3D68, ConfTotal=3D31 =
after 9 queries ( typically - results vary ).

So this seems to work well enough in practice, however it seems somewhat =
arbitrary, and thus not entirely satisfactory, leaving open potential =
inter-operability problems.

The standards aspect is that implementors of authoritative DNS servers =
could be warned that non-deterministic responses may cause some =
resolvers to make multiple repeat requests, leading to either loss of =
performance and increased traffic, or reduced security, if resolvers =
decide to accept data below a safe entropy level.

It's not entirely clear to me what such servers are trying to achieve, =
but I suspect it could be achieved by changing the served data on a =
slightly less frequent basis ( for example once a minute rather than on =
every request ). An alternative would be to use long names, which allows =
extra entropy to be encoded via the 0x20 channel, eliminating the need =
for repeat queries, or to implement other proposals for increasing =
entropy ( e.g. AL record ).

I don't believe such servers are common, so "fixing" them may be =
possible. It could be that akamai is the only significant example - =
although I certainly don't know this, Has anyone researched this? It is =
impossible to update ALL authoritative servers, however updating most of =
the significant non-deterministic ones may be feasible in a reasonable =
time frame, and that is should be good enough.

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	charset="iso-8859-1"
Content-Transfer-Encoding: quoted-printable

<!DOCTYPE HTML PUBLIC "-//W3C//DTD HTML 4.0 Transitional//EN">
<HTML><HEAD>
<META http-equiv=3DContent-Type content=3D"text/html; =
charset=3Diso-8859-1">
<META content=3D"MSHTML 6.00.6000.16705" name=3DGENERATOR>
<STYLE></STYLE>
</HEAD>
<BODY bgColor=3D#ffffff>
<DIV><FONT face=3DArial size=3D2>When sending a repeat request ( to =
increase entropy=20
), some name servers give different replies on each =
request.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>Has anyone considered the best way to =
handle this?=20
</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>My current heuristic is to =
count</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>Total =3D Total number of distinct =
records=20
seen.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2>ConfTotal =3D Total number of distinct =
records=20
confirmed ( total entropy above threshold of 50 bits ).</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>and to stop when</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>Total &gt; 0 and Total =3D =
ConfTotal&nbsp;// the=20
normal case for deterministic servers</FONT></DIV>
<DIV><FONT face=3DArial size=3D2>or </FONT><FONT face=3DArial =
size=3D2>ConfTotal &gt;=20
30</FONT></DIV>
<DIV><FONT face=3DArial size=3D2>or in any case after 20 =
queries.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>An example is found when resolving the =
host=20
E120.G.AKAMAIEDGE.NET</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>Using the heuristic above, this stops =
with=20
Total=3D68, ConfTotal=3D31 after 9 queries ( typically - results vary=20
).</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>So this seems to work well enough in =
practice,=20
however it seems somewhat arbitrary, and thus not entirely satisfactory, =
leaving=20
open potential inter-operability problems.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>The standards aspect is =
that&nbsp;implementors of=20
authoritative DNS servers could be warned that non-deterministic =
responses may=20
cause&nbsp;some resolvers to make multiple repeat requests, leading to =
either=20
loss of performance and&nbsp;increased traffic, or reduced security, if=20
resolvers decide to accept data below a safe&nbsp;entropy =
level.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>It's not entirely clear to me what such =
servers are=20
trying to achieve, but I suspect it could be achieved by changing the =
served=20
data on a slightly less frequent basis ( for example once a minute =
rather than=20
on every request ). </FONT><FONT face=3DArial size=3D2>An alternative =
would=20
be&nbsp;to use long names, which allows extra entropy to be encoded via =
the 0x20=20
channel, eliminating the need for repeat queries, or to implement other=20
proposals for increasing entropy ( e.g. AL record ).</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT><FONT face=3DArial =
size=3D2></FONT>&nbsp;</DIV>
<DIV><FONT face=3DArial size=3D2>I don't believe such servers are =
common,&nbsp;so=20
"fixing" them may be possible.&nbsp;It could be that akamai is the only=20
significant example - although I certainly don't know this, Has anyone=20
researched this? I</FONT><FONT face=3DArial size=3D2>t is impossible =
to&nbsp;update=20
ALL authoritative servers, however updating most of the significant=20
non-deterministic ones may be feasible in a reasonable time frame, and =
that=20
is&nbsp;should be&nbsp;good enough.</FONT></DIV>
<DIV><FONT face=3DArial size=3D2></FONT>&nbsp;</DIV></BODY></HTML>

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From owner-namedroppers@ops.ietf.org  Sun Aug 31 05:50:28 2008
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From: Francis Dupont <Francis.Dupont@fdupont.fr>
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Subject: Re: dnscurve -- new or did I just miss this? 
In-reply-to: Your message of Sat, 30 Aug 2008 23:43:10 -0000.
             <20080830234310.GA17717@pwns.ms> 
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 In your previous mail you wrote:

  so there is little motivation to moving to elliptic curves.
   
=> I disagree:
 - ECs are faster than RSA and give smaller keys and signatures
 - ECs are based on a different mechanism than RSA, it is important
  to provide a choice between two basic mechanisms in case one of
  them is discovered far too weak (note this applies too to a EC
  only solution :-)
So IMHO it should be good to investigate about an ECDSA DNSSEC option.

Regards

Francis.Dupont@fdupont.fr

PS: cryptographers I know promote the use of ECs...

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From owner-namedroppers@ops.ietf.org  Sun Aug 31 06:02:48 2008
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From: David Dagon <dagon@cc.gatech.edu>
To: Florian Weimer <fweimer@bfk.de>
Cc: Paul Vixie <vixie@isc.org>, Stephane Bortzmeyer <bortzmeyer@nic.fr>,
        Jim Reid <jim@rfc1035.com>,
        Nicholas Weaver <nweaver@ICSI.Berkeley.EDU>,
        Namedroppers <namedroppers@ops.ietf.org>
Subject: Re: New Version Notification for draft-reid-dnsext-aleatoric-00
Message-ID: <20080831125411.GB66937@fritz.cc.gt.atl.ga.us>
References: <20080828152751.GA21778@nic.fr> <43486DCC-FA35-447B-BF1C-914A20429562@rfc1035.com> <FD632403-A4B6-4245-B420-478B5F00AE53@icsi.berkeley.edu> <04928188-0DE7-4259-81DB-94469B7CE39F@rfc1035.com> <26223.1219958219@nsa.vix.com> <20080829074209.GA15508@nic.fr> <88896.1220025059@nsa.vix.com> <82hc93py7e.fsf@mid.bfk.de> <617.1220029414@nsa.vix.com> <827i9zpukh.fsf@mid.bfk.de>
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On Fri, Aug 29, 2008 at 08:03:42PM +0200, Florian Weimer wrote:
<quoting answer>
> 
> > i hope this clarifies the BCP 79 status of dns-0x20.
> 
> Yes, thank you very much.

Sorry, I overlooked your previous inquiry.  

I have no intention of patenting or copyrighting DNS-0x20.  

I have taken numerous steps to resist such efforts.  I have written
(and will shortly present) a paper on DNS-0x20, which destroys any
hopes of international or US-based intellectual property rights.  And
public talks I give on the topic all note that DNS-0x20 is
patent-free.

Thus, none of the organizations I work for could make a colorable
claim otherwise.  I believe I've made it impossible for one to claim
patents of copyrights on DNS-0x20.

-- 
David Dagon              /"\                          "When cryptography
dagon@cc.gatech.edu      \ /  ASCII RIBBON CAMPAIGN    is outlawed, bayl
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From owner-namedroppers@ops.ietf.org  Sun Aug 31 06:47:40 2008
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From: Francis Dupont <Francis.Dupont@fdupont.fr>
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draft-hubert-ulevitch-edns-ping-00.txt should mention the PING EDNS0
option is a first class cover channel in its "Security Considerations".

Francis.Dupont@fdupont.fr

PS: I don't say it is a bad thing...

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From owner-namedroppers@ops.ietf.org  Sun Aug 31 08:14:08 2008
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Subject: Re: dnscurve -- new or did I just miss this? 
Date: Sun, 31 Aug 2008 08:05:19 -0700
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On Aug 31, 2008, at 5:38 AM, Francis Dupont wrote:

> In your previous mail you wrote:
>
> so there is little motivation to moving to elliptic curves.
>
> => I disagree:
> - ECs are faster than RSA and give smaller keys and signatures

This is true.  Especially if you want to maintain for, as much as  
possible, the DNS maximum message size over UDP.


> - ECs are based on a different mechanism than RSA, it is important
> to provide a choice between two basic mechanisms in case one of
> them is discovered far too weak (note this applies too to a EC
> only solution :-)

This I disagree with.

Although the elliptic curve discrete log problem (and the discrete log  
problem in general) are separate from the factoring problem, every  
breakthrough in one almost invariably produces a breakthrough in the  
other.

Of special worry is quantum computing, which affects ECC just the same  
as RSA, and is actually a footnote in the original quantum computing  
beats factoring paper.


Additionaly, there was a big discussion of this very problem at the  
AES candidate meeting in the "choose 1 algorithm or 2" discussion. In  
general, the crptographer's consensus is that only a single algorithm  
should be chosen, as actually specifying two opens up more  
vulnerabilities than a fallback provision provides.


Frankly speaking, the markeplace reason for a competitor to DNSSEC has  
to arrise from ease-of-use concerns, not choice of crypto.


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From owner-namedroppers@ops.ietf.org  Sun Aug 31 08:15:05 2008
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To: George Barwood <george.barwood@blueyonder.co.uk>
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On Aug 31, 2008, at 12:35 AM, George Barwood wrote:
> When sending a repeat request ( to increase entropy ), some name  
> servers give different replies on each request.
>
> Has anyone considered the best way to handle this?

This is why I advocate treating cache and transaction separately.  EG,  
assume you are behind a NAT, so you only have 0x20, and you're looking  
for a typical 8 character name.  Thus you only have 24 bits of  
entropy, which is uncomfortably low.

If you send two requests and, if they disagree, don't cache the result  
but do return (a random) result with a TTL of 1 second, the name will  
have resolved with 23b of entropy, but the cache will be protected  
with 47b of entropy.


This is because blind transaction attacks are really limited:  you  
need to trick the victim into issuing a request and acting on it  
immediately at the application layer, which is a much smaller window  
than a cache attack.

Thus the consequence:  As long as the authority always sends  
disagreeing results, each result is individually protected by a 23b  
race.  But such races are transactional attacks, which are far less  
useful than cache attacks.

As soon as it returns an agreeing results, it gets cached with 47b of  
entropy, which means its infeasible for a blind cache attack.


> It's not entirely clear to me what such servers are trying to  
> achieve, but I suspect it could be achieved by changing the served  
> data on a slightly less frequent basis ( for example once a minute  
> rather than on every request ). An alternative would be to use long  
> names, which allows extra entropy to be encoded via the 0x20  
> channel, eliminating the need for repeat queries, or to implement  
> other proposals for increasing entropy ( e.g. AL record ).

Since a lot of this is for load-balancing purposes, expect that this  
volatility will remain.

You won't get them to change, but I argue it is SAFE to accept them  
for transactions as opposed to caching.


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Subject: Re: dnscurve -- new or did I just miss this?
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On Aug 30, 2008, at 7:43 PM, list-namedroppers@pwns.ms wrote:

>> But it has some interesting ideas.  I am not a crypto guy, so maybe I
>> am wrong, but could we use that elliptic curve cryptography in place
>> of RSA?
>
> I think so. RFC4034 defines algorithim number 4 for elliptic curves,  
> but I don't see any definition for it's usage.

There isn't one that made it through last call, but there is a  
proposed definition.  See: http://tools.ietf.org/wg/dnsext/draft-ietf-dnsext-ecc-key/

There was the thought that this proposal was too wide open and thus  
too complex.  However, no one has (yet) published a DNSKEY proposal  
for a simpler version, or pushed harder for the existing version to  
move forward.

--
David Blacka                          <davidb@verisign.com>
Sr. Engineer                   Platform Product Development


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             <96E7F32A-84A6-4481-A6D2-0CB4999C26F5@icsi.berkeley.edu> 
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> ...
> If you send two requests and, if they disagree, don't cache the result
> but do return (a random) result with a TTL of 1 second, the name will
> have resolved with 23b of entropy, but the cache will be protected with
> 47b of entropy.
> ...

as also noted privately, a TTL of 0 on the RDNS response is useful in this
case since if the response goes to a forwarder rather than to a stub we
would not want it reused even for the remainder of that 1 second period.

> ...
> Thus the consequence: As long as the authority always sends disagreeing
> results, each result is individually protected by a 23b race.  But such
> races are transactional attacks, which are far less useful than cache
> attacks.
> ...

i note with amusement that servers who send disagreeing results usually have
very short TTLs (five seconds) and would probably enjoy it if we shortened
them still further.  these are mostly load balancers who do not benefit from
caching in the ramparts.  they don't use TTL 0 because it's considered rude
when an ADNS does that.  but if an RDNS does it, hey, who are they to argue?

> As soon as it returns an agreeing results, it gets cached with 47b of
> entropy, which means its infeasible for a blind cache attack.

this is a very neat solution to the problem i couldn't find a solution for
in my "minimum entropy" proposal a month or so ago.

> ... I argue it is SAFE to accept them for transactions as opposed to
> caching.

safety is in the eye of the beholder.  if someone is behind a NAT
derandomizer and they have 24 bits of entropy then they have a lot less
than ten hours between successful keyhole attacks and they ought to worry.
in that sense, your proposal makes them safer, and that's worth noting.
(of course, stopping the derandomization of source-port would also make
them safer.)

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From owner-namedroppers@ops.ietf.org  Sun Aug 31 10:02:12 2008
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Subject: Re: Repeat queries to non-deterministic servers
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> Thus the consequence:  As long as the authority always sends  disagreeing 
> results, each result is individually protected by a 23b  race.  But such 
> races are transactional attacks, which are far less  useful than cache 
> attacks.

If I can have it, I prefer to have 50 bits everywhere, and a simple design 
where everything gets cached.

> Since a lot of this is for load-balancing purposes, expect that this 
> volatility will remain.

For load balancing, it's not necessary to have complete non-determinism ( 
albeit this may be the easy option ).

> You won't get them to change....

I probably wrongly gave the impression that I NEED them to change. In this 
case the records involved are NS records with a relatively long TTL ( 30 
minutes ), and once established in the cache, can be refreshed with a single 
query.

It all works absolutely fine in practice, and the extra traffic is 
completely insignificant, so the inefficiency is very theoretical.
The A records (which are deterministic) have a TTL of 20 seconds, so these 
can be expected to dominate the load.

If I understand your proposal correctly, each time one of these 20 second 
TTL A records expire, 2 requests would be needed instead of 1, as the 
non-deterministic NS record will not have been cached. That would produce a 
far higher extra load.

Another consideration : any genuine operational problems (with the 
convergence algorithm given) will I think only occur in the context of huge 
server farms. So if there are problems, I think they will come to light very 
rapidly. There cannot be too many organisations with networks of 
hundres/thousands of nameservers, so if Akamai are the largest, I think any 
problem is likely to be theoretical. Must do some more surfing :)



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From owner-namedroppers@ops.ietf.org  Sun Aug 31 13:33:47 2008
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[I posted a variation on this message as a comment on Dan Kaminsky's 
blog earlier today, but I'm skeptical he'll have the time to respond, so 
I'm throwing it out to a wider audience.]

So here's a question. With source port randomization, what prevents the 
following attack?

Attacker sets up a nameserver for example.com that receives queries but 
sends no responses, with an appropriate delegation. Attacker then asks 
the victim nameserver ~2^16 distinct queries under example.com in a 
short time frame. This effectively consumes the entire source port range 
with outstanding queries. The example.com nameserver observes the source 
port for each inbound recursive query from the victim nameserver; the 
one remaining source port that was not observed is the only port left to 
the victim nameserver for its next query. Attacker then asks victim 
nameserver for the domain to be poisoned, and forges the poison response 
targeting the remaining port.

I'm presenting an idealized attack here for the purpose of illustration. 
The principle is to deplete the entropy included in source port 
randomization by consuming the majority of available ports with 
outstanding queries. The attack would only be effective against a 
nameserver that allows close to 2^16 outstanding queries, i.e. high open 
file descriptor limit, FD_SETSIZE appropriately redefined, etc.; a 
nameserver that could have only 1024 outstanding requests, for example, 
would be DoSed before it would lose significant entropy. The outstanding 
requests could be distributed among many domains and distinct 
nameservers if necessary, as long as the nameservers coordinate. The 
attack could be partly mitigated on nameservers that allow ~2^16 
outstanding requests if the victim nameserver can reuse randomly chosen, 
already open sockets for multiple successive requests once ~2^16 ports 
are bound. The efficacy of this attack depends on the precise algorithm 
by which the victim uses new ports, and what limits are enforced.

I have to wonder how this has been addressed in the various resolvers 
that implement source port randomization. Where has this scenario been 
discussed before? It's too obvious not to have been considered earlier, 
but I've done some Googling and skimmed some list archives and haven't 
come up with anything.

-- 
Jefferson Ogata : Internetworker, Antibozo

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To: "Blacka, David" <davidb@verisign.com>
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Subject: Re: dnscurve -- new or did I just miss this?
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References: <48B9AE7C.4070703@everydns.net> <e90946380808301452t7257f3f4tfd375c41f47fb560@mail.gmail.com> <20080830223839.GA15555@pwns.ms> <e90946380808301628t4b176172vea77dd4dcf148cda@mail.gmail.com> <20080830234310.GA17717@pwns.ms> <215F9FF8-1BCB-472E-B91F-263510C202EF@verisign.com>
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On Sun, Aug 31, 2008 at 11:33:52AM -0400,
 Blacka, David <davidb@verisign.com> wrote 
 a message of 27 lines which said:

> There isn't one that made it through last call, but there is a proposed 
> definition.  See: 
> http://tools.ietf.org/wg/dnsext/draft-ietf-dnsext-ecc-key/

Warning, we are deriving into a general discussion on EC cryptography
and this thread, IMHO, should stay focused on DNScurve.

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Subject: Re: dnscurve -- new or did I just miss this?
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References: <48B9AE7C.4070703@everydns.net> <e90946380808301452t7257f3f4tfd375c41f47fb560@mail.gmail.com> <20080830223839.GA15555@pwns.ms> <e90946380808301628t4b176172vea77dd4dcf148cda@mail.gmail.com> <20080830234310.GA17717@pwns.ms> <215F9FF8-1BCB-472E-B91F-263510C202EF@verisign.com> <20080831204429.GA12465@sources.org>
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On Sun, Aug 31, 2008 at 10:44:29PM +0200, Stephane Bortzmeyer wrote:
> > definition.  See: 
> > http://tools.ietf.org/wg/dnsext/draft-ietf-dnsext-ecc-key/
> 
> Warning, we are deriving into a general discussion on EC cryptography
> and this thread, IMHO, should stay focused on DNScurve.

Ah yes, very good. Ok - about there being no trust anchors, I don't think
this is explicit in the design. They just haven't been mentioned yet, but
I'm pretty sure they could be added out of band - for people who want to be
really sure.

	Bert

-- 
http://www.PowerDNS.com      Open source, database driven DNS Software 
http://netherlabs.nl              Open and Closed source services

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> Frankly speaking, the markeplace reason for a competitor to DNSSEC has  
> to arrise from ease-of-use concerns, not choice of crypto.

ease of use being an engineering problem, it seems quite soluble to me.

however, if we're going to reconsider "how to secure dns" and are therefore
willing to throw away the last 13 or so years of work and ditch the products
and vendors in this nascent industry, then i'd like it if masataka ohta's
proposal was also considered.

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From owner-namedroppers@ops.ietf.org  Sun Aug 31 16:35:18 2008
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To: Jefferson Ogata <bind-users@antibozo.net>
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: Outstanding queries vs. source port randomization entropy 
In-reply-to: Your message of "Sun, 31 Aug 2008 20:24:47 GMT."
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> [I posted a variation on this message as a comment on Dan Kaminsky's 
> blog earlier today, but I'm skeptical he'll have the time to respond, so 
> I'm throwing it out to a wider audience.]
> 
> So here's a question. With source port randomization, what prevents the 
> following attack?
> 
> Attacker sets up a nameserver for example.com that receives queries but 
> sends no responses, with an appropriate delegation. Attacker then asks 
> the victim nameserver ~2^16 distinct queries under example.com in a 
> short time frame. This effectively consumes the entire source port range 
> with outstanding queries. The example.com nameserver observes the source 
> port for each inbound recursive query from the victim nameserver; the 
> one remaining source port that was not observed is the only port left to 
> the victim nameserver for its next query. Attacker then asks victim 
> nameserver for the domain to be poisoned, and forges the poison response 
> targeting the remaining port.
> 
> I'm presenting an idealized attack here for the purpose of illustration. 
> The principle is to deplete the entropy included in source port 
> randomization by consuming the majority of available ports with 
> outstanding queries. The attack would only be effective against a 
> nameserver that allows close to 2^16 outstanding queries, i.e. high open 
> file descriptor limit, FD_SETSIZE appropriately redefined, etc.; a 
> nameserver that could have only 1024 outstanding requests, for example, 
> would be DoSed before it would lose significant entropy. The outstanding 
> requests could be distributed among many domains and distinct 
> nameservers if necessary, as long as the nameservers coordinate. The 
> attack could be partly mitigated on nameservers that allow ~2^16 
> outstanding requests if the victim nameserver can reuse randomly chosen, 
> already open sockets for multiple successive requests once ~2^16 ports 
> are bound. The efficacy of this attack depends on the precise algorithm 
> by which the victim uses new ports, and what limits are enforced.
> 
> I have to wonder how this has been addressed in the various resolvers 
> that implement source port randomization. Where has this scenario been 
> discussed before? It's too obvious not to have been considered earlier, 
> but I've done some Googling and skimmed some list archives and haven't 
> come up with anything.
> 
> -- 
> Jefferson Ogata : Internetworker, Antibozo
> 
> --
> to unsubscribe send a message to namedroppers-request@ops.ietf.org with
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	Use connected UDP socket then kernel can also use the source
	address as a differentiator when delivering replies.  You
	can then support <ports> x <txid> to an individual destination.

	You still need to randomly select ports and randomly select
	txid.  When you have a collision you just need to repick
	one and/or the other.   A port collision alone lets you use
	a existing socket.

	For queries to another server you just set SO_REUSEADDR
	when you have a port collision with a port you already have
	open as the existing one is in a connected state.  If it
	is a port that is not already in use you don't set SO_REUSEADDR
	so you detect collisions with other applications.
	
	Mark
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Sun Aug 31 16:44:49 2008
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On 2008-08-31 23:26, Mark Andrews wrote:
> Jefferson Ogata wrote [attribution restored]:
>>  The 
>> attack could be partly mitigated on nameservers that allow ~2^16 
>> outstanding requests if the victim nameserver can reuse randomly chosen, 
>> already open sockets for multiple successive requests once ~2^16 ports 
>> are bound.
>>
> 	You still need to randomly select ports and randomly select
> 	txid.  When you have a collision you just need to repick
> 	one and/or the other.   A port collision alone lets you use
> 	a existing socket.

I believe I considered that possibility in the above part of my comment. 
The question in that case remains: does any existing resolver that 
supports source port randomization actually do this?

> 	For queries to another server you just set SO_REUSEADDR
> 	when you have a port collision with a port you already have
> 	open as the existing one is in a connected state.  If it
> 	is a port that is not already in use you don't set SO_REUSEADDR
> 	so you detect collisions with other applications.

I don't see why you need SO_REUSEADDR. Why not simply leave the UDP port 
unconnected and use sendto in the first place?

-- 
Jefferson Ogata : Internetworker, Antibozo

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From owner-namedroppers@ops.ietf.org  Sun Aug 31 17:08:21 2008
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Subject: Re: dnscurve -- new or did I just miss this? 
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At Sun, 31 Aug 2008 08:05:19 -0700,
Nicholas Weaver wrote:
>=20
>=20
> On Aug 31, 2008, at 5:38 AM, Francis Dupont wrote:
>=20
> > In your previous mail you wrote:
> >
> > so there is little motivation to moving to elliptic curves.
> >
> > =3D> I disagree:
> > - ECs are faster than RSA and give smaller keys and signatures
>=20
> This is true.  Especially if you want to maintain for, as much as =20
> possible, the DNS maximum message size over UDP.

It's not clear to me that signing computational performance is a
particularly major factor here, since DNSSEC is designed to avoid the
need for the signature to be recomputed for each request served, so
the only per-transaction overhead is verification. RSA verification is
extremely fast. For instance, on my MacBook Air, a single 1024-bit RSA
verification takes about 500us. Note that EC verification is actually
quite a bit slower than RSA verification up to large key sizes, so
this isn't an advantage of EC, really.

ISTM that the primary advantage of EC in DNSSEC is compactness
of representation:

         Pubkey Size (bits)        Signature Size (bits)
RSA                   1024*                         1024
ECDSA                 160**                        320**

*  Assumes that e is fixed, e.g., to F4. Otherwise, you need
   1-3 bytes to represent e
** With point compression and a single fixed EC curve.


There are other tradeoffs you can make. For instance, if all you care
about is signature size, you can do quite a bit better here. BLS
[BLS04] is a pairing-based signature scheme that has a 160-bit
signature.  An additional BLS benefit is that you can aggregate the
signatures.  I.e., you can produce a single signature that is 160-bits
long that combines two signatures by different signers, which lets you
compress signature chains.

Unfortunately, BLS verification performance is quite a bit slower than
RSA verification, probably more like RSA signing (I'm guessing order
25 ms, but I don't have current data). This doesn't seem like a real
problem for endhosts, but could certainly be one for recursive
resolvers. Also, the public keys are fairly large so it's not
clear that the public key + signature size is better than ECDSA.

FWIW Looking at dnscurve, it doesn't look like a signature-based
syste at all. Rather, the client and server do a DH exchange and use the=20
DH shared secret to authenticate the data. This has a number of
obvious drawbacks in the DNS setting, including inability to
cache and online vulnerability of the server to private key
theft.

-Ekr


[BLS04] Dan Boneh, Ben Lynn, and Hovav Shacham, "Short Signatures
from the Weil Pairing", J. Cryptology, 17(4):297?319, Sep. 2004.




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To: Jefferson Ogata <bind-users@antibozo.net>
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: Outstanding queries vs. source port randomization entropy 
In-reply-to: Your message of "Sun, 31 Aug 2008 23:35:49 GMT."
             <48BB2AD5.7090402@antibozo.net> 
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> On 2008-08-31 23:26, Mark Andrews wrote:
> > Jefferson Ogata wrote [attribution restored]:
> >>  The 
> >> attack could be partly mitigated on nameservers that allow ~2^16 
> >> outstanding requests if the victim nameserver can reuse randomly chosen, 
> >> already open sockets for multiple successive requests once ~2^16 ports 
> >> are bound.
> >>
> > 	You still need to randomly select ports and randomly select
> > 	txid.  When you have a collision you just need to repick
> > 	one and/or the other.   A port collision alone lets you use
> > 	a existing socket.
> 
> I believe I considered that possibility in the above part of my comment. 
> The question in that case remains: does any existing resolver that 
> supports source port randomization actually do this?
> 
> > 	For queries to another server you just set SO_REUSEADDR
> > 	when you have a port collision with a port you already have
> > 	open as the existing one is in a connected state.  If it
> > 	is a port that is not already in use you don't set SO_REUSEADDR
> > 	so you detect collisions with other applications.
> 
> I don't see why you need SO_REUSEADDR. Why not simply leave the UDP port 
> unconnected and use sendto in the first place?

	Because you really want to have the kernel do the initial
	filtering of responses.  You don't want your recursive
	server seeing every stray UDP packet being sent to you.
	With the amount of malware out there that is trying to get
	in over UDP your recursive server will be getting lots of
	noise if you randomly choose such a port.  Connected sockets
	don't interfere with other uses of UDP (e.g. traceroute).
	You can't probe to see what ports are in use by the recursive
	server without making the server actually make queries to
	you.

	Mark
 
> -- 
> Jefferson Ogata : Internetworker, Antibozo
> 
> --
> to unsubscribe send a message to namedroppers-request@ops.ietf.org with
> the word 'unsubscribe' in a single line as the message text body.
> archive: <http://ops.ietf.org/lists/namedroppers/>
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Sun Aug 31 17:59:52 2008
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From: Jefferson Ogata <bind-users@antibozo.net>
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To: namedroppers@ops.ietf.org
Subject: Re: Outstanding queries vs. source port randomization entropy
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On 2008-09-01 00:30, Mark Andrews wrote:
>> On 2008-08-31 23:26, Mark Andrews wrote:
>>> Jefferson Ogata wrote [attribution restored]:
>> I don't see why you need SO_REUSEADDR. Why not simply leave the UDP port 
>> unconnected and use sendto in the first place?
> 
> 	Because you really want to have the kernel do the initial
> 	filtering of responses.  You don't want your recursive
> 	server seeing every stray UDP packet being sent to you.
> 	With the amount of malware out there that is trying to get
> 	in over UDP your recursive server will be getting lots of
> 	noise if you randomly choose such a port.  Connected sockets
> 	don't interfere with other uses of UDP (e.g. traceroute).
> 	You can't probe to see what ports are in use by the recursive
> 	server without making the server actually make queries to
> 	you.

I see. That clarifies it. So, since you're writing from ISC, does BIND 
do this, or is it on the roadmap if not?

-- 
Jefferson Ogata : Internetworker, Antibozo

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Cc: Jefferson Ogata <bind-users@antibozo.net>, namedroppers@ops.ietf.org
From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: Outstanding queries vs. source port randomization entropy 
In-reply-to: Your message of "Mon, 01 Sep 2008 10:30:18 +1000."
Date: Mon, 01 Sep 2008 10:46:59 +1000
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> 
> > On 2008-08-31 23:26, Mark Andrews wrote:
> > > Jefferson Ogata wrote [attribution restored]:
> > >>  The 
> > >> attack could be partly mitigated on nameservers that allow ~2^16 
> > >> outstanding requests if the victim nameserver can reuse randomly chosen,
>  
> > >> already open sockets for multiple successive requests once ~2^16 ports 
> > >> are bound.
> > >>
> > > 	You still need to randomly select ports and randomly select
> > > 	txid.  When you have a collision you just need to repick
> > > 	one and/or the other.   A port collision alone lets you use
> > > 	a existing socket.
> > 
> > I believe I considered that possibility in the above part of my comment. 
> > The question in that case remains: does any existing resolver that 
> > supports source port randomization actually do this?
> > 
> > > 	For queries to another server you just set SO_REUSEADDR
> > > 	when you have a port collision with a port you already have
> > > 	open as the existing one is in a connected state.  If it
> > > 	is a port that is not already in use you don't set SO_REUSEADDR
> > > 	so you detect collisions with other applications.
> > 
> > I don't see why you need SO_REUSEADDR. Why not simply leave the UDP port 
> > unconnected and use sendto in the first place?
> 
> 	Because you really want to have the kernel do the initial
> 	filtering of responses.  You don't want your recursive
> 	server seeing every stray UDP packet being sent to you.
> 	With the amount of malware out there that is trying to get
> 	in over UDP your recursive server will be getting lots of
> 	noise if you randomly choose such a port.  Connected sockets
> 	don't interfere with other uses of UDP (e.g. traceroute).
> 	You can't probe to see what ports are in use by the recursive
> 	server without making the server actually make queries to
> 	you.
> 
> 	Mark

	Additionally with sendto() you will tend to get locked onto
	a open set of ports as you need to wait for the next response
	whenever you re-use a port.  With connect() each transaction
	becomes almost completely independent of other transaction.

	Note all the probability analysis being done assume
	independent transactions.  If you have depenancies between
	transactions (i.e. re-use of a socket) then all the analyses
	needs to be redone to factor in that socket re-use.

	Even without doing such a analysis I can tell you that
	re-use makes the system weaker not stronger.

	Mark

> > -- 
> > Jefferson Ogata : Internetworker, Antibozo
> > 
> > --
> > to unsubscribe send a message to namedroppers-request@ops.ietf.org with
> > the word 'unsubscribe' in a single line as the message text body.
> > archive: <http://ops.ietf.org/lists/namedroppers/>
> -- 
> Mark Andrews, ISC
> 1 Seymour St., Dundas Valley, NSW 2117, Australia
> PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org
-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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From owner-namedroppers@ops.ietf.org  Sun Aug 31 18:11:38 2008
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From: Jefferson Ogata <bind-users@antibozo.net>
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Subject: Re: Outstanding queries vs. source port randomization entropy
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On 2008-09-01 00:46, Mark Andrews wrote:
> 	Additionally with sendto() you will tend to get locked onto
> 	a open set of ports as you need to wait for the next response
> 	whenever you re-use a port.  With connect() each transaction
> 	becomes almost completely independent of other transaction.

I don't follow; when you have ~2^16 distinct source ports bound, how can 
you get locked into a sub-optimal set of ports?

Your point about combining connected UDP sockets with SO_REUSEADDR in 
order to take advantage of kernel filtering and avoid impacting on other 
uses of UDP is well taken, but a drawback I see is that your file 
descriptor set has to continue to grow past 2^16 if you don't actually 
reuse existing sockets.

> 	Note all the probability analysis being done assume
> 	independent transactions.  If you have depenancies between
> 	transactions (i.e. re-use of a socket) then all the analyses
> 	needs to be redone to factor in that socket re-use.
> 
> 	Even without doing such a analysis I can tell you that
> 	re-use makes the system weaker not stronger.

I only speculate about reuse of source ports as mitigation against the 
complete loss of source port entropy once the number of free source 
ports becomes small. I.e. the source port would continue to be random 
regardless of the size of the pool of available source ports. I don't 
see how this makes the system weaker; what am I missing?

-- 
Jefferson Ogata : Internetworker, Antibozo

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From owner-namedroppers@ops.ietf.org  Sun Aug 31 18:39:47 2008
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Mark Andrews wrote:
>>
>> <no-hat>
>> At 14:24 20/08/2008, Paul Vixie wrote:
>>>>> i propose that an empty answer be sent
>>>> What can stand as an empty answer?  REFUSED?
>>> ANCOUNT=0
>> RCODE=REFUSED seems to me to be a cleaner solution and as nameserver
>> are allowed to send that back any time it likes, this is not even a
>> hit of protocol change.
>> Someone can just write a short document
>> "QTYPE=ANY considered harmful, just REFUSE them"  :-)
>> to document the practice and point the people at that complain.
> 
> 	We have load balancers that send REFUSED rather than NOERROR
> 	for AAAA queries today.  These cause operational problems.
>  

It seems to me that we have the classic problem of responses written for 
servers based on certain conditions leaving the clients to try and 
figure out what that response really meant. What is really needed is a 
document that says the response X will happen under the following list 
of circumstances, and response Y will happen under these other 
circumstances. Then it becomes easy to figure out what is the most 
appropriate response based on some new circumstances. Clients need to 
understand the meaning of the response within the context of the query.

Danny


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To: Jefferson Ogata <bind-users@antibozo.net>
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From: Mark Andrews <Mark_Andrews@isc.org>
Subject: Re: Outstanding queries vs. source port randomization entropy 
In-reply-to: Your message of "Mon, 01 Sep 2008 01:02:58 GMT."
             <48BB3F42.7030305@antibozo.net> 
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> On 2008-09-01 00:46, Mark Andrews wrote:
> > 	Additionally with sendto() you will tend to get locked onto
> > 	a open set of ports as you need to wait for the next response
> > 	whenever you re-use a port.  With connect() each transaction
> > 	becomes almost completely independent of other transaction.
> 
> I don't follow; when you have ~2^16 distinct source ports bound, how can 
> you get locked into a sub-optimal set of ports?

	Ususally you don't have 2^16 ports in use.
	
> Your point about combining connected UDP sockets with SO_REUSEADDR in 
> order to take advantage of kernel filtering and avoid impacting on other 
> uses of UDP is well taken, but a drawback I see is that your file 
> descriptor set has to continue to grow past 2^16 if you don't actually 
> reuse existing sockets.

	Yes.  There are tradeoffs everywhere in this space.
 
	Mark

-- 
Mark Andrews, ISC
1 Seymour St., Dundas Valley, NSW 2117, Australia
PHONE: +61 2 9871 4742                 INTERNET: Mark_Andrews@isc.org

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Date: Mon, 01 Sep 2008 03:33:05 +0000
From: Jefferson Ogata <bind-users@antibozo.net>
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To: namedroppers@ops.ietf.org
Subject: Re: Outstanding queries vs. source port randomization entropy
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On 2008-09-01 01:44, Mark Andrews wrote:
> Jefferson Ogata wrote [attribution restored, again--dude, you should fix that]:
>> On 2008-09-01 00:46, Mark Andrews wrote:
>>> 	Additionally with sendto() you will tend to get locked onto
>>> 	a open set of ports as you need to wait for the next response
>>> 	whenever you re-use a port.  With connect() each transaction
>>> 	becomes almost completely independent of other transaction.
>> I don't follow; when you have ~2^16 distinct source ports bound, how can 
>> you get locked into a sub-optimal set of ports?
> 
> 	Ususally you don't have 2^16 ports in use.

Well, yes, in which case, you are just using new ports as usual. Am I 
being very unclear?

Really, the optimal behavior would be to choose the source port for the 
next query based strictly on your entropy source, and not on 
availability at all. So once you pass 2^15 outstanding queries, you 
would be more likely to reuse a source port than not to, if you want to 
maintain unpredictability of source port numbers.

So it seems to me that any implementation that is not designed to reuse 
source ports, even at a very low rate when there are only a few 
outstanding queries, is not optimizing the entropy available in source 
port randomization.

-- 
Jefferson Ogata : Internetworker, Antibozo

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