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References: <7500672F-5BDE-4EBE-ABC3-1AFEF2972D95@vpnc.org> <70E51AD3-D937-416E-8F3C-60B6156190DC@vpnc.org> <CAMm+LwgSrwBO=cD5zQ5G1PG0YyC7gvG7cWGqhL1KhPectG6Y+w@mail.gmail.com> <DDDF8726-F491-46AB-9A4A-AFB99006A393@vpnc.org> <42F98BCB-17F8-427E-8E9D-33A04978A339@vpnc.org> <CAMm+LwihwHFYcAkJvjRe7Js9AJkS8s6ZooxJnE526UOsWHGCuw@mail.gmail.com> <A09B4DFF-936C-488C-9915-B5F9A579FA1F@vpnc.org> <CABrd9STFeAxxmFDCZMkREXyEcKbeeQbF8ZeESXcoKPnkckdZwQ@mail.gmail.com> <CAMm+Lwg6EoSy-p7US0uZtKjxGHF39iH-0mvxg-hJ+AqK4vXL-A@mail.gmail.com> <CABrd9SRa9Ye9gkjpaQ+PqQyay9NKJB__dkDwOBwPHvw16dkTRg@mail.gmail.com> <544B0DD62A64C1448B2DA253C0114146069D3FBAE8@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM> <CAOuvq22PMSq2sAmUBfJcWu6LhEdCA3jKteu38m4UuHbykp7xZw@mail.gmail.com> <544B0DD62A64C1448B2DA253C0114146069D5FC685@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM> <6DD8CB4F-1233-403D-A27E-F3F80310390F@vpnc.org> <544B0DD62A64C1448B2DA253C0114146069D5FC79B@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM> <508A48C5.9070005@comodo.com> <CABrd9SR4y5nRm-AP6t5_HzUO+CROwh+KnVn48_9hMTFQ4A93=Q@mail.gmail.com> <544B0DD62A64C1448B2DA253C0114146069D76E5FC@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM> <CABrd9STHtw__Wm30Z5T27mx8PMb-mScCSa-EZVDdeQvy_Rru1Q@mail.gmail.com> <544B0DD62A64C1448B2DA253C0114146069F66F830@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM>
Date: Thu, 1 Nov 2012 09:10:28 +0000
Message-ID: <CABrd9SSJWm_8BY9uN4D6=LmogwkNeLMZtJaOX2MQU1QuCHJwyg@mail.gmail.com>
From: Ben Laurie <benl@google.com>
To: Rick Andrews <Rick_Andrews@symantec.com>
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Cc: "therightkey@ietf.org" <therightkey@ietf.org>, Rob Stradling <rob.stradling@comodo.com>, Paul Hoffman <paul.hoffman@vpnc.org>
Subject: Re: [therightkey] Other solutions to the problem
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On 31 October 2012 23:57, Rick Andrews <Rick_Andrews@symantec.com> wrote:
>> -----Original Message-----
>> From: Ben Laurie [mailto:benl@google.com]
>> Sent: Monday, October 29, 2012 3:10 AM
>> To: Rick Andrews
>> Cc: Rob Stradling; therightkey@ietf.org; Paul Hoffman
>> Subject: Re: [therightkey] Other solutions to the problem
>>
>> On 26 October 2012 22:31, Rick Andrews <Rick_Andrews@symantec.com>
>> wrote:
>> >> -----Original Message-----
>> >> From: Ben Laurie [mailto:benl@google.com]
>> >> Sent: Friday, October 26, 2012 1:51 AM
>> >> To: Rob Stradling
>> >> Cc: Rick Andrews; therightkey@ietf.org; Paul Hoffman
>> >> Subject: Re: [therightkey] Other solutions to the problem
>> >>
>> >> On 26 October 2012 09:24, Rob Stradling <rob.stradling@comodo.com>
>> >> wrote:
>> >> > On 26/10/12 00:58, Rick Andrews wrote:
>> >> > <snip>
>> >> >
>> >> >> AFAICT, for CT to really work it will require participation from
>> >> every CA
>> >> >> whose roots are in browsers. I think you're underestimating how
>> hard
>> >> it will
>> >> >> be to achieve that.
>> >> >
>> >> >
>> >> > Rick,
>> >> >
>> >> > Ultimately, assuming the RFC5878 TLS extension gains widespread
>> >> support in
>> >> > server and client software, CT won't _require_ participation from
>> any
>> >> CA.
>> >> > Each certificate holder will be able to configure their server to
>> >> send their
>> >> > certificate's CT proof to each client.
>> >
>> > I see, so the certificate holder can submit their newly-minted
>> certificate to a log server to get a CT proof. Instead of requiring the
>> participation of every CA, you now require the participation of every
>> certificate holder.
>>
>> No, it is an option.
>
> I understand that. I was trying to point out that for CT to be effective,=
 you either need all CAs to participate, or for every CA that doesn't parti=
cipate, their customers who want protection have to participate directly. I=
 feel that's a pretty high bar to surmount.

Its only software. The process of participating in CT for a server operator=
 is:

1. Run command line tool once, giving it your certificate as input and
an SCT file as output.

2. Add one line of configuration to your server config.

Not exactly rocket science. If people _really_ find it hard, we could
build it into the servers so there was no manual step at all.

>> >You might say that not every certificate holder will need or want CT,
>> but I would guess that the number that would want the protection would
>> be far greater than the number of CAs.
>>
>> Given that the plan is browsers will refuse non-CTed certs, I imagine
>> most holder of certificates used by the public will want CT.
>
> Do you have agreements with the major browser vendors to do this? It's po=
ssible that not all of them will be on board.

In practice, only one major browser needs to participate to give herd
immunity. Obviously it would be nice if they all did, but it is not an
urgent problem.

>> >> > But with participation from the CAs, it should be possible to
>> realize
>> >> the CT
>> >> > dream far sooner.  And (even in a future world where RFC5878 is
>> >> supported
>> >> > everywhere) if the CA takes care of CT proof distribution, then
>> that
>> >> makes
>> >> > life easier for the certificate holder.
>> >> >
>> >> >
>> >> >> Further, no one has yet brought up the privacy issue. CAs sell a
>> lot
>> >> of
>> >> >> certificates to companies for their internal use. Some of them
>> may
>> >> object to
>> >> >> publishing all their internal domain names.
>> >> >
>> >> >
>> >> > This has been a concern for Comodo too, so I spoke to AGL about it
>> a
>> >> few
>> >> > weeks ago.  AIUI, the plan is that CT clients will have a user-
>> >> configurable
>> >> > whitelist (empty by default) of domain names for which CT proofs
>> will
>> >> not be
>> >> > required.  Participating CAs should allow customers to opt-out
>> from
>> >> having
>> >> > their certs automatically logged with CT.
>> >
>> > I believe in your plan each browser will be a CT client. Aside from
>> the fact that the white list is an attractive target for hackers, I
>> don't see how the average user is going to know how to configure this
>> white list. I'm reminded of Adam's arguments against Convergence
>> (http://www.imperialviolet.org/2011/09/07/convergence.html).
>>
>> This is why I think the best solution is to issue private certs
>> through a name constrained intermediate which is logged.
>
> I agree.

I'm glad we agree on something!

From hallam@gmail.com  Thu Nov  1 04:22:48 2012
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References: <7500672F-5BDE-4EBE-ABC3-1AFEF2972D95@vpnc.org> <70E51AD3-D937-416E-8F3C-60B6156190DC@vpnc.org> <CAMm+LwgSrwBO=cD5zQ5G1PG0YyC7gvG7cWGqhL1KhPectG6Y+w@mail.gmail.com> <DDDF8726-F491-46AB-9A4A-AFB99006A393@vpnc.org> <42F98BCB-17F8-427E-8E9D-33A04978A339@vpnc.org> <CAMm+LwihwHFYcAkJvjRe7Js9AJkS8s6ZooxJnE526UOsWHGCuw@mail.gmail.com> <A09B4DFF-936C-488C-9915-B5F9A579FA1F@vpnc.org> <CABrd9STFeAxxmFDCZMkREXyEcKbeeQbF8ZeESXcoKPnkckdZwQ@mail.gmail.com> <CAMm+Lwg6EoSy-p7US0uZtKjxGHF39iH-0mvxg-hJ+AqK4vXL-A@mail.gmail.com> <CABrd9SRa9Ye9gkjpaQ+PqQyay9NKJB__dkDwOBwPHvw16dkTRg@mail.gmail.com> <544B0DD62A64C1448B2DA253C0114146069D3FBAE8@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM> <CAOuvq22PMSq2sAmUBfJcWu6LhEdCA3jKteu38m4UuHbykp7xZw@mail.gmail.com> <544B0DD62A64C1448B2DA253C0114146069D5FC685@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM> <6DD8CB4F-1233-403D-A27E-F3F80310390F@vpnc.org> <544B0DD62A64C1448B2DA253C0114146069D5FC79B@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM> <508A48C5.9070005@comodo.com> <CABrd9SR4y5nRm-AP6t5_HzUO+CROwh+KnVn48_9hMTFQ4A93=Q@mail.gmail.com> <544B0DD62A64C1448B2DA253C0114146069D76E5FC@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM> <CABrd9STHtw__Wm30Z5T27mx8PMb-mScCSa-EZVDdeQvy_Rru1Q@mail.gmail.com> <544B0DD62A64C1448B2DA253C0114146069F66F830@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM> <CABrd9SSJWm_8BY9uN4D6=LmogwkNeLMZtJaOX2MQU1QuCHJwyg@mail.gmail.com>
Date: Thu, 1 Nov 2012 07:22:46 -0400
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From: Phillip Hallam-Baker <hallam@gmail.com>
To: Ben Laurie <benl@google.com>
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Cc: "therightkey@ietf.org" <therightkey@ietf.org>, Rob Stradling <rob.stradling@comodo.com>, Paul Hoffman <paul.hoffman@vpnc.org>, Rick Andrews <Rick_Andrews@symantec.com>
Subject: Re: [therightkey] Other solutions to the problem
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Zero net admin steps is probably a necessary criteria. What you think not
hard might as well be rocket science to most.


On Thu, Nov 1, 2012 at 5:10 AM, Ben Laurie <benl@google.com> wrote:

> On 31 October 2012 23:57, Rick Andrews <Rick_Andrews@symantec.com> wrote:
> >> -----Original Message-----
> >> From: Ben Laurie [mailto:benl@google.com]
> >> Sent: Monday, October 29, 2012 3:10 AM
> >> To: Rick Andrews
> >> Cc: Rob Stradling; therightkey@ietf.org; Paul Hoffman
> >> Subject: Re: [therightkey] Other solutions to the problem
> >>
> >> On 26 October 2012 22:31, Rick Andrews <Rick_Andrews@symantec.com>
> >> wrote:
> >> >> -----Original Message-----
> >> >> From: Ben Laurie [mailto:benl@google.com]
> >> >> Sent: Friday, October 26, 2012 1:51 AM
> >> >> To: Rob Stradling
> >> >> Cc: Rick Andrews; therightkey@ietf.org; Paul Hoffman
> >> >> Subject: Re: [therightkey] Other solutions to the problem
> >> >>
> >> >> On 26 October 2012 09:24, Rob Stradling <rob.stradling@comodo.com>
> >> >> wrote:
> >> >> > On 26/10/12 00:58, Rick Andrews wrote:
> >> >> > <snip>
> >> >> >
> >> >> >> AFAICT, for CT to really work it will require participation from
> >> >> every CA
> >> >> >> whose roots are in browsers. I think you're underestimating how
> >> hard
> >> >> it will
> >> >> >> be to achieve that.
> >> >> >
> >> >> >
> >> >> > Rick,
> >> >> >
> >> >> > Ultimately, assuming the RFC5878 TLS extension gains widespread
> >> >> support in
> >> >> > server and client software, CT won't _require_ participation from
> >> any
> >> >> CA.
> >> >> > Each certificate holder will be able to configure their server to
> >> >> send their
> >> >> > certificate's CT proof to each client.
> >> >
> >> > I see, so the certificate holder can submit their newly-minted
> >> certificate to a log server to get a CT proof. Instead of requiring the
> >> participation of every CA, you now require the participation of every
> >> certificate holder.
> >>
> >> No, it is an option.
> >
> > I understand that. I was trying to point out that for CT to be
> effective, you either need all CAs to participate, or for every CA that
> doesn't participate, their customers who want protection have to
> participate directly. I feel that's a pretty high bar to surmount.
>
> Its only software. The process of participating in CT for a server
> operator is:
>
> 1. Run command line tool once, giving it your certificate as input and
> an SCT file as output.
>
> 2. Add one line of configuration to your server config.
>
> Not exactly rocket science. If people _really_ find it hard, we could
> build it into the servers so there was no manual step at all.
>
> >> >You might say that not every certificate holder will need or want CT,
> >> but I would guess that the number that would want the protection would
> >> be far greater than the number of CAs.
> >>
> >> Given that the plan is browsers will refuse non-CTed certs, I imagine
> >> most holder of certificates used by the public will want CT.
> >
> > Do you have agreements with the major browser vendors to do this? It's
> possible that not all of them will be on board.
>
> In practice, only one major browser needs to participate to give herd
> immunity. Obviously it would be nice if they all did, but it is not an
> urgent problem.
>
> >> >> > But with participation from the CAs, it should be possible to
> >> realize
> >> >> the CT
> >> >> > dream far sooner.  And (even in a future world where RFC5878 is
> >> >> supported
> >> >> > everywhere) if the CA takes care of CT proof distribution, then
> >> that
> >> >> makes
> >> >> > life easier for the certificate holder.
> >> >> >
> >> >> >
> >> >> >> Further, no one has yet brought up the privacy issue. CAs sell a
> >> lot
> >> >> of
> >> >> >> certificates to companies for their internal use. Some of them
> >> may
> >> >> object to
> >> >> >> publishing all their internal domain names.
> >> >> >
> >> >> >
> >> >> > This has been a concern for Comodo too, so I spoke to AGL about it
> >> a
> >> >> few
> >> >> > weeks ago.  AIUI, the plan is that CT clients will have a user-
> >> >> configurable
> >> >> > whitelist (empty by default) of domain names for which CT proofs
> >> will
> >> >> not be
> >> >> > required.  Participating CAs should allow customers to opt-out
> >> from
> >> >> having
> >> >> > their certs automatically logged with CT.
> >> >
> >> > I believe in your plan each browser will be a CT client. Aside from
> >> the fact that the white list is an attractive target for hackers, I
> >> don't see how the average user is going to know how to configure this
> >> white list. I'm reminded of Adam's arguments against Convergence
> >> (http://www.imperialviolet.org/2011/09/07/convergence.html).
> >>
> >> This is why I think the best solution is to issue private certs
> >> through a name constrained intermediate which is logged.
> >
> > I agree.
>
> I'm glad we agree on something!
> _______________________________________________
> therightkey mailing list
> therightkey@ietf.org
> https://www.ietf.org/mailman/listinfo/therightkey
>



-- 
Website: http://hallambaker.com/

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Zero net admin steps is probably a necessary criteria. What you think not h=
ard might as well be rocket science to most.<div class=3D"gmail_extra"><br>=
<br><div class=3D"gmail_quote">On Thu, Nov 1, 2012 at 5:10 AM, Ben Laurie <=
span dir=3D"ltr">&lt;<a href=3D"mailto:benl@google.com" target=3D"_blank">b=
enl@google.com</a>&gt;</span> wrote:<br>
<blockquote class=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1p=
x #ccc solid;padding-left:1ex"><div class=3D"HOEnZb"><div class=3D"h5">On 3=
1 October 2012 23:57, Rick Andrews &lt;<a href=3D"mailto:Rick_Andrews@syman=
tec.com">Rick_Andrews@symantec.com</a>&gt; wrote:<br>

&gt;&gt; -----Original Message-----<br>
&gt;&gt; From: Ben Laurie [mailto:<a href=3D"mailto:benl@google.com">benl@g=
oogle.com</a>]<br>
&gt;&gt; Sent: Monday, October 29, 2012 3:10 AM<br>
&gt;&gt; To: Rick Andrews<br>
&gt;&gt; Cc: Rob Stradling; <a href=3D"mailto:therightkey@ietf.org">therigh=
tkey@ietf.org</a>; Paul Hoffman<br>
&gt;&gt; Subject: Re: [therightkey] Other solutions to the problem<br>
&gt;&gt;<br>
&gt;&gt; On 26 October 2012 22:31, Rick Andrews &lt;<a href=3D"mailto:Rick_=
Andrews@symantec.com">Rick_Andrews@symantec.com</a>&gt;<br>
&gt;&gt; wrote:<br>
&gt;&gt; &gt;&gt; -----Original Message-----<br>
&gt;&gt; &gt;&gt; From: Ben Laurie [mailto:<a href=3D"mailto:benl@google.co=
m">benl@google.com</a>]<br>
&gt;&gt; &gt;&gt; Sent: Friday, October 26, 2012 1:51 AM<br>
&gt;&gt; &gt;&gt; To: Rob Stradling<br>
&gt;&gt; &gt;&gt; Cc: Rick Andrews; <a href=3D"mailto:therightkey@ietf.org"=
>therightkey@ietf.org</a>; Paul Hoffman<br>
&gt;&gt; &gt;&gt; Subject: Re: [therightkey] Other solutions to the problem=
<br>
&gt;&gt; &gt;&gt;<br>
&gt;&gt; &gt;&gt; On 26 October 2012 09:24, Rob Stradling &lt;<a href=3D"ma=
ilto:rob.stradling@comodo.com">rob.stradling@comodo.com</a>&gt;<br>
&gt;&gt; &gt;&gt; wrote:<br>
&gt;&gt; &gt;&gt; &gt; On 26/10/12 00:58, Rick Andrews wrote:<br>
&gt;&gt; &gt;&gt; &gt; &lt;snip&gt;<br>
&gt;&gt; &gt;&gt; &gt;<br>
&gt;&gt; &gt;&gt; &gt;&gt; AFAICT, for CT to really work it will require pa=
rticipation from<br>
&gt;&gt; &gt;&gt; every CA<br>
&gt;&gt; &gt;&gt; &gt;&gt; whose roots are in browsers. I think you&#39;re =
underestimating how<br>
&gt;&gt; hard<br>
&gt;&gt; &gt;&gt; it will<br>
&gt;&gt; &gt;&gt; &gt;&gt; be to achieve that.<br>
&gt;&gt; &gt;&gt; &gt;<br>
&gt;&gt; &gt;&gt; &gt;<br>
&gt;&gt; &gt;&gt; &gt; Rick,<br>
&gt;&gt; &gt;&gt; &gt;<br>
&gt;&gt; &gt;&gt; &gt; Ultimately, assuming the RFC5878 TLS extension gains=
 widespread<br>
&gt;&gt; &gt;&gt; support in<br>
&gt;&gt; &gt;&gt; &gt; server and client software, CT won&#39;t _require_ p=
articipation from<br>
&gt;&gt; any<br>
&gt;&gt; &gt;&gt; CA.<br>
&gt;&gt; &gt;&gt; &gt; Each certificate holder will be able to configure th=
eir server to<br>
&gt;&gt; &gt;&gt; send their<br>
&gt;&gt; &gt;&gt; &gt; certificate&#39;s CT proof to each client.<br>
&gt;&gt; &gt;<br>
&gt;&gt; &gt; I see, so the certificate holder can submit their newly-minte=
d<br>
&gt;&gt; certificate to a log server to get a CT proof. Instead of requirin=
g the<br>
&gt;&gt; participation of every CA, you now require the participation of ev=
ery<br>
&gt;&gt; certificate holder.<br>
&gt;&gt;<br>
&gt;&gt; No, it is an option.<br>
&gt;<br>
&gt; I understand that. I was trying to point out that for CT to be effecti=
ve, you either need all CAs to participate, or for every CA that doesn&#39;=
t participate, their customers who want protection have to participate dire=
ctly. I feel that&#39;s a pretty high bar to surmount.<br>

<br>
</div></div>Its only software. The process of participating in CT for a ser=
ver operator is:<br>
<br>
1. Run command line tool once, giving it your certificate as input and<br>
an SCT file as output.<br>
<br>
2. Add one line of configuration to your server config.<br>
<br>
Not exactly rocket science. If people _really_ find it hard, we could<br>
build it into the servers so there was no manual step at all.<br>
<div class=3D"im"><br>
&gt;&gt; &gt;You might say that not every certificate holder will need or w=
ant CT,<br>
&gt;&gt; but I would guess that the number that would want the protection w=
ould<br>
&gt;&gt; be far greater than the number of CAs.<br>
&gt;&gt;<br>
&gt;&gt; Given that the plan is browsers will refuse non-CTed certs, I imag=
ine<br>
&gt;&gt; most holder of certificates used by the public will want CT.<br>
&gt;<br>
&gt; Do you have agreements with the major browser vendors to do this? It&#=
39;s possible that not all of them will be on board.<br>
<br>
</div>In practice, only one major browser needs to participate to give herd=
<br>
immunity. Obviously it would be nice if they all did, but it is not an<br>
urgent problem.<br>
<div><div class=3D"h5"><br>
&gt;&gt; &gt;&gt; &gt; But with participation from the CAs, it should be po=
ssible to<br>
&gt;&gt; realize<br>
&gt;&gt; &gt;&gt; the CT<br>
&gt;&gt; &gt;&gt; &gt; dream far sooner. =A0And (even in a future world whe=
re RFC5878 is<br>
&gt;&gt; &gt;&gt; supported<br>
&gt;&gt; &gt;&gt; &gt; everywhere) if the CA takes care of CT proof distrib=
ution, then<br>
&gt;&gt; that<br>
&gt;&gt; &gt;&gt; makes<br>
&gt;&gt; &gt;&gt; &gt; life easier for the certificate holder.<br>
&gt;&gt; &gt;&gt; &gt;<br>
&gt;&gt; &gt;&gt; &gt;<br>
&gt;&gt; &gt;&gt; &gt;&gt; Further, no one has yet brought up the privacy i=
ssue. CAs sell a<br>
&gt;&gt; lot<br>
&gt;&gt; &gt;&gt; of<br>
&gt;&gt; &gt;&gt; &gt;&gt; certificates to companies for their internal use=
. Some of them<br>
&gt;&gt; may<br>
&gt;&gt; &gt;&gt; object to<br>
&gt;&gt; &gt;&gt; &gt;&gt; publishing all their internal domain names.<br>
&gt;&gt; &gt;&gt; &gt;<br>
&gt;&gt; &gt;&gt; &gt;<br>
&gt;&gt; &gt;&gt; &gt; This has been a concern for Comodo too, so I spoke t=
o AGL about it<br>
&gt;&gt; a<br>
&gt;&gt; &gt;&gt; few<br>
&gt;&gt; &gt;&gt; &gt; weeks ago. =A0AIUI, the plan is that CT clients will=
 have a user-<br>
&gt;&gt; &gt;&gt; configurable<br>
&gt;&gt; &gt;&gt; &gt; whitelist (empty by default) of domain names for whi=
ch CT proofs<br>
&gt;&gt; will<br>
&gt;&gt; &gt;&gt; not be<br>
&gt;&gt; &gt;&gt; &gt; required. =A0Participating CAs should allow customer=
s to opt-out<br>
&gt;&gt; from<br>
&gt;&gt; &gt;&gt; having<br>
&gt;&gt; &gt;&gt; &gt; their certs automatically logged with CT.<br>
&gt;&gt; &gt;<br>
&gt;&gt; &gt; I believe in your plan each browser will be a CT client. Asid=
e from<br>
&gt;&gt; the fact that the white list is an attractive target for hackers, =
I<br>
&gt;&gt; don&#39;t see how the average user is going to know how to configu=
re this<br>
&gt;&gt; white list. I&#39;m reminded of Adam&#39;s arguments against Conve=
rgence<br>
&gt;&gt; (<a href=3D"http://www.imperialviolet.org/2011/09/07/convergence.h=
tml" target=3D"_blank">http://www.imperialviolet.org/2011/09/07/convergence=
.html</a>).<br>
&gt;&gt;<br>
&gt;&gt; This is why I think the best solution is to issue private certs<br=
>
&gt;&gt; through a name constrained intermediate which is logged.<br>
&gt;<br>
&gt; I agree.<br>
<br>
</div></div>I&#39;m glad we agree on something!<br>
<div class=3D"HOEnZb"><div class=3D"h5">___________________________________=
____________<br>
therightkey mailing list<br>
<a href=3D"mailto:therightkey@ietf.org">therightkey@ietf.org</a><br>
<a href=3D"https://www.ietf.org/mailman/listinfo/therightkey" target=3D"_bl=
ank">https://www.ietf.org/mailman/listinfo/therightkey</a><br>
</div></div></blockquote></div><br><br clear=3D"all"><div><br></div>-- <br>=
Website: <a href=3D"http://hallambaker.com/">http://hallambaker.com/</a><br=
><br>
</div>

--e89a8fb1f72c14ab6e04cd6d3d61--

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Date: Thu, 1 Nov 2012 11:26:36 +0000
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From: Ben Laurie <benl@google.com>
To: Phillip Hallam-Baker <hallam@gmail.com>
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Cc: "therightkey@ietf.org" <therightkey@ietf.org>, Rob Stradling <rob.stradling@comodo.com>, Paul Hoffman <paul.hoffman@vpnc.org>, Rick Andrews <Rick_Andrews@symantec.com>
Subject: Re: [therightkey] Other solutions to the problem
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On 1 November 2012 11:22, Phillip Hallam-Baker <hallam@gmail.com> wrote:
> Zero net admin steps is probably a necessary criteria. What you think not
> hard might as well be rocket science to most.

Maybe, but the rocket science involved in getting a cert in the first
place is far worse.

>
>
> On Thu, Nov 1, 2012 at 5:10 AM, Ben Laurie <benl@google.com> wrote:
>>
>> On 31 October 2012 23:57, Rick Andrews <Rick_Andrews@symantec.com> wrote:
>> >> -----Original Message-----
>> >> From: Ben Laurie [mailto:benl@google.com]
>> >> Sent: Monday, October 29, 2012 3:10 AM
>> >> To: Rick Andrews
>> >> Cc: Rob Stradling; therightkey@ietf.org; Paul Hoffman
>> >> Subject: Re: [therightkey] Other solutions to the problem
>> >>
>> >> On 26 October 2012 22:31, Rick Andrews <Rick_Andrews@symantec.com>
>> >> wrote:
>> >> >> -----Original Message-----
>> >> >> From: Ben Laurie [mailto:benl@google.com]
>> >> >> Sent: Friday, October 26, 2012 1:51 AM
>> >> >> To: Rob Stradling
>> >> >> Cc: Rick Andrews; therightkey@ietf.org; Paul Hoffman
>> >> >> Subject: Re: [therightkey] Other solutions to the problem
>> >> >>
>> >> >> On 26 October 2012 09:24, Rob Stradling <rob.stradling@comodo.com>
>> >> >> wrote:
>> >> >> > On 26/10/12 00:58, Rick Andrews wrote:
>> >> >> > <snip>
>> >> >> >
>> >> >> >> AFAICT, for CT to really work it will require participation from
>> >> >> every CA
>> >> >> >> whose roots are in browsers. I think you're underestimating how
>> >> hard
>> >> >> it will
>> >> >> >> be to achieve that.
>> >> >> >
>> >> >> >
>> >> >> > Rick,
>> >> >> >
>> >> >> > Ultimately, assuming the RFC5878 TLS extension gains widespread
>> >> >> support in
>> >> >> > server and client software, CT won't _require_ participation from
>> >> any
>> >> >> CA.
>> >> >> > Each certificate holder will be able to configure their server to
>> >> >> send their
>> >> >> > certificate's CT proof to each client.
>> >> >
>> >> > I see, so the certificate holder can submit their newly-minted
>> >> certificate to a log server to get a CT proof. Instead of requiring the
>> >> participation of every CA, you now require the participation of every
>> >> certificate holder.
>> >>
>> >> No, it is an option.
>> >
>> > I understand that. I was trying to point out that for CT to be
>> > effective, you either need all CAs to participate, or for every CA that
>> > doesn't participate, their customers who want protection have to participate
>> > directly. I feel that's a pretty high bar to surmount.
>>
>> Its only software. The process of participating in CT for a server
>> operator is:
>>
>> 1. Run command line tool once, giving it your certificate as input and
>> an SCT file as output.
>>
>> 2. Add one line of configuration to your server config.
>>
>> Not exactly rocket science. If people _really_ find it hard, we could
>> build it into the servers so there was no manual step at all.
>>
>> >> >You might say that not every certificate holder will need or want CT,
>> >> but I would guess that the number that would want the protection would
>> >> be far greater than the number of CAs.
>> >>
>> >> Given that the plan is browsers will refuse non-CTed certs, I imagine
>> >> most holder of certificates used by the public will want CT.
>> >
>> > Do you have agreements with the major browser vendors to do this? It's
>> > possible that not all of them will be on board.
>>
>> In practice, only one major browser needs to participate to give herd
>> immunity. Obviously it would be nice if they all did, but it is not an
>> urgent problem.
>>
>> >> >> > But with participation from the CAs, it should be possible to
>> >> realize
>> >> >> the CT
>> >> >> > dream far sooner.  And (even in a future world where RFC5878 is
>> >> >> supported
>> >> >> > everywhere) if the CA takes care of CT proof distribution, then
>> >> that
>> >> >> makes
>> >> >> > life easier for the certificate holder.
>> >> >> >
>> >> >> >
>> >> >> >> Further, no one has yet brought up the privacy issue. CAs sell a
>> >> lot
>> >> >> of
>> >> >> >> certificates to companies for their internal use. Some of them
>> >> may
>> >> >> object to
>> >> >> >> publishing all their internal domain names.
>> >> >> >
>> >> >> >
>> >> >> > This has been a concern for Comodo too, so I spoke to AGL about it
>> >> a
>> >> >> few
>> >> >> > weeks ago.  AIUI, the plan is that CT clients will have a user-
>> >> >> configurable
>> >> >> > whitelist (empty by default) of domain names for which CT proofs
>> >> will
>> >> >> not be
>> >> >> > required.  Participating CAs should allow customers to opt-out
>> >> from
>> >> >> having
>> >> >> > their certs automatically logged with CT.
>> >> >
>> >> > I believe in your plan each browser will be a CT client. Aside from
>> >> the fact that the white list is an attractive target for hackers, I
>> >> don't see how the average user is going to know how to configure this
>> >> white list. I'm reminded of Adam's arguments against Convergence
>> >> (http://www.imperialviolet.org/2011/09/07/convergence.html).
>> >>
>> >> This is why I think the best solution is to issue private certs
>> >> through a name constrained intermediate which is logged.
>> >
>> > I agree.
>>
>> I'm glad we agree on something!
>> _______________________________________________
>> therightkey mailing list
>> therightkey@ietf.org
>> https://www.ietf.org/mailman/listinfo/therightkey
>
>
>
>
> --
> Website: http://hallambaker.com/
>

From paul.hoffman@vpnc.org  Thu Nov  1 08:14:58 2012
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Subject: [therightkey] Barely-capable CAs
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On Nov 1, 2012, at 2:10 AM, Ben Laurie <benl@google.com> wrote:

> Its only software. The process of participating in CT for a server =
operator is:
>=20
> 1. Run command line tool once, giving it your certificate as input and
> an SCT file as output.
>=20
> 2. Add one line of configuration to your server config.
>=20
> Not exactly rocket science. If people _really_ find it hard, we could
> build it into the servers so there was no manual step at all.

As someone who has to trust every CA in the root pile in my browsers and =
OSs, I find it frightening that a CA who can say "this is your bank's =
certificate" cannot handle new requirements for how to say that. If =
adopting a simple protocol like this causes an ossified CA too many =
problems, maybe I don't trust that CA to be able to issue certificates =
for my bank, much less to be able to know which certificates that they =
are actually issuing.

--Paul Hoffman=

From hallam@gmail.com  Thu Nov  1 09:29:37 2012
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Date: Thu, 1 Nov 2012 12:29:31 -0400
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From: Phillip Hallam-Baker <hallam@gmail.com>
To: Paul Hoffman <paul.hoffman@vpnc.org>
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Cc: "therightkey@ietf.org" <therightkey@ietf.org>
Subject: Re: [therightkey] Barely-capable CAs
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This is about barely capable sysadmins.

Different problem.


On Thu, Nov 1, 2012 at 11:14 AM, Paul Hoffman <paul.hoffman@vpnc.org> wrote:

> On Nov 1, 2012, at 2:10 AM, Ben Laurie <benl@google.com> wrote:
>
> > Its only software. The process of participating in CT for a server
> operator is:
> >
> > 1. Run command line tool once, giving it your certificate as input and
> > an SCT file as output.
> >
> > 2. Add one line of configuration to your server config.
> >
> > Not exactly rocket science. If people _really_ find it hard, we could
> > build it into the servers so there was no manual step at all.
>
> As someone who has to trust every CA in the root pile in my browsers and
> OSs, I find it frightening that a CA who can say "this is your bank's
> certificate" cannot handle new requirements for how to say that. If
> adopting a simple protocol like this causes an ossified CA too many
> problems, maybe I don't trust that CA to be able to issue certificates for
> my bank, much less to be able to know which certificates that they are
> actually issuing.
>
> --Paul Hoffman
> _______________________________________________
> therightkey mailing list
> therightkey@ietf.org
> https://www.ietf.org/mailman/listinfo/therightkey
>



-- 
Website: http://hallambaker.com/

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This is about barely capable sysadmins.=A0<div><br></div><div>Different pro=
blem.</div><div class=3D"gmail_extra"><br><br><div class=3D"gmail_quote">On=
 Thu, Nov 1, 2012 at 11:14 AM, Paul Hoffman <span dir=3D"ltr">&lt;<a href=
=3D"mailto:paul.hoffman@vpnc.org" target=3D"_blank">paul.hoffman@vpnc.org</=
a>&gt;</span> wrote:<br>
<blockquote class=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1p=
x #ccc solid;padding-left:1ex">On Nov 1, 2012, at 2:10 AM, Ben Laurie &lt;<=
a href=3D"mailto:benl@google.com">benl@google.com</a>&gt; wrote:<br>
<br>
&gt; Its only software. The process of participating in CT for a server ope=
rator is:<br>
&gt;<br>
&gt; 1. Run command line tool once, giving it your certificate as input and=
<br>
&gt; an SCT file as output.<br>
&gt;<br>
&gt; 2. Add one line of configuration to your server config.<br>
&gt;<br>
&gt; Not exactly rocket science. If people _really_ find it hard, we could<=
br>
&gt; build it into the servers so there was no manual step at all.<br>
<br>
As someone who has to trust every CA in the root pile in my browsers and OS=
s, I find it frightening that a CA who can say &quot;this is your bank&#39;=
s certificate&quot; cannot handle new requirements for how to say that. If =
adopting a simple protocol like this causes an ossified CA too many problem=
s, maybe I don&#39;t trust that CA to be able to issue certificates for my =
bank, much less to be able to know which certificates that they are actuall=
y issuing.<br>

<span class=3D"HOEnZb"><font color=3D"#888888"><br>
--Paul Hoffman<br>
_______________________________________________<br>
therightkey mailing list<br>
<a href=3D"mailto:therightkey@ietf.org">therightkey@ietf.org</a><br>
<a href=3D"https://www.ietf.org/mailman/listinfo/therightkey" target=3D"_bl=
ank">https://www.ietf.org/mailman/listinfo/therightkey</a><br>
</font></span></blockquote></div><br><br clear=3D"all"><div><br></div>-- <b=
r>Website: <a href=3D"http://hallambaker.com/">http://hallambaker.com/</a><=
br><br>
</div>

--f46d044630781c335e04cd7186be--

From llynch@civil-tongue.net  Thu Nov  1 09:38:34 2012
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Cc: "therightkey@ietf.org" <therightkey@ietf.org>, Paul Hoffman <paul.hoffman@vpnc.org>
Subject: Re: [therightkey] Barely-capable CAs
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On Thu, 1 Nov 2012, Phillip Hallam-Baker wrote:

> This is about barely capable sysadmins.

I'm a barely capable sysadmin and the steps Ben outlined seem both 
reasonable and do-able to me. I also like the option to build it into the 
server where smart hands can build it into the default options for 
configuration -

- Lucy

> Different problem.
>
>
> On Thu, Nov 1, 2012 at 11:14 AM, Paul Hoffman <paul.hoffman@vpnc.org> wrote:
>
>> On Nov 1, 2012, at 2:10 AM, Ben Laurie <benl@google.com> wrote:
>>
>>> Its only software. The process of participating in CT for a server
>> operator is:
>>>
>>> 1. Run command line tool once, giving it your certificate as input and
>>> an SCT file as output.
>>>
>>> 2. Add one line of configuration to your server config.
>>>
>>> Not exactly rocket science. If people _really_ find it hard, we could
>>> build it into the servers so there was no manual step at all.
>>
>> As someone who has to trust every CA in the root pile in my browsers and
>> OSs, I find it frightening that a CA who can say "this is your bank's
>> certificate" cannot handle new requirements for how to say that. If
>> adopting a simple protocol like this causes an ossified CA too many
>> problems, maybe I don't trust that CA to be able to issue certificates for
>> my bank, much less to be able to know which certificates that they are
>> actually issuing.
>>
>> --Paul Hoffman
>> _______________________________________________
>> therightkey mailing list
>> therightkey@ietf.org
>> https://www.ietf.org/mailman/listinfo/therightkey
>>
>
>
>
>
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_______________________________________________
therightkey mailing list
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https://www.ietf.org/mailman/listinfo/therightkey

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From: Paul Hoffman <paul.hoffman@vpnc.org>
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Subject: Re: [therightkey] Barely-capable CAs
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On Nov 1, 2012, at 9:29 AM, Phillip Hallam-Baker <hallam@gmail.com> =
wrote:

> This is about barely capable sysadmins.=20
>=20
> Different problem.

=46rom the perspective of the relying party (me, caring about making a =
secure connection to my bank), the problems are indistinguishable. A CA =
who retains a sysadmin who is barely capable deserves less trust than =
one who retains sysadmins who are capable.

My bank, when trying to decide which CAs might get removed from the root =
piles in the future, should also see the problems as indistinguishable. =
That is, I would hope that my bank would pick a CA who is capable and =
non-ossified so that, when the incapable and ossified CAs are removed =
from the root piles, my bank doesn't need to get a new cert.

I would not mind if adoption of certificate transparency hastens the =
shedding of barely-capable CAs; the one-time hassle for some users would =
be far outweighed by the longer-term benefit to the security of the =
Internet.

--Paul Hoffman=

From Rick_Andrews@symantec.com  Thu Nov  1 10:08:20 2012
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From: Rick Andrews <Rick_Andrews@symantec.com>
To: Paul Hoffman <paul.hoffman@vpnc.org>, "therightkey@ietf.org" <therightkey@ietf.org>
Date: Thu, 1 Nov 2012 10:08:14 -0700
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Subject: Re: [therightkey] Barely-capable CAs
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> -----Original Message-----
> From: therightkey-bounces@ietf.org [mailto:therightkey-
> bounces@ietf.org] On Behalf Of Paul Hoffman
> Sent: Thursday, November 01, 2012 8:15 AM
> To: therightkey@ietf.org
> Subject: [therightkey] Barely-capable CAs
>=20
> On Nov 1, 2012, at 2:10 AM, Ben Laurie <benl@google.com> wrote:
>=20
> > Its only software. The process of participating in CT for a server
> operator is:
> >
> > 1. Run command line tool once, giving it your certificate as input
> and
> > an SCT file as output.
> >
> > 2. Add one line of configuration to your server config.
> >
> > Not exactly rocket science. If people _really_ find it hard, we could
> > build it into the servers so there was no manual step at all.
>=20
> As someone who has to trust every CA in the root pile in my browsers
> and OSs, I find it frightening that a CA who can say "this is your
> bank's certificate" cannot handle new requirements for how to say that.
> If adopting a simple protocol like this causes an ossified CA too many
> problems, maybe I don't trust that CA to be able to issue certificates
> for my bank, much less to be able to know which certificates that they
> are actually issuing.

Paul, I find your statements to be oversimplifications:

1) That the CT protocol is simple: I've been trying to make the point on th=
is list that it may be conceptually simple but pretty difficult to implemen=
t to the scale that is required.

2) That CAs can't handle new requirements: I'm not convinced that CT is the=
 silver bullet that some appear to claim it is. If you were referring to my=
 statements on this list, please don't interpret my criticism as inability =
to handle new requirements. I think a debate on the merits is healthy.

-Rick

From hallam@gmail.com  Thu Nov  1 10:22:37 2012
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From: Phillip Hallam-Baker <hallam@gmail.com>
To: Lucy Lynch <llynch@civil-tongue.net>
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Cc: "therightkey@ietf.org" <therightkey@ietf.org>, Paul Hoffman <paul.hoffman@vpnc.org>
Subject: Re: [therightkey] Barely-capable CAs
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>From my perspective it is much cheaper for me to build a tool that does the
job right and give it to you than to follow the usual approach of yet more
poorly designed and documented stuff that might work or might not.

Having worked in Web security over 20 years now, I have still to see a case
where a system was breached because of a really subtle design flaw. Every
security issue I have seen has been really simple once it has been
identified and isolated.

Computer systems are hard to run and harder to secure because of the volume
of complexity rather than the degree of complexity. Each individual step is
trivial in itself but the cumulative effect is very large. I am sitting
next to the print edition of the Oxford English Dictionary which is 20
volumes of dense print. It is something like 200Mb in total. That was the
pinacle of achievement of Victorian research taking several decades and
thousands of authors. Modern operating systems and applications are much
larger. And because we design and build them in the wrong way it only takes
one mistake for them to fail.

One way that real world sysops defend themselves against complexity is to
refuse to learn anything that is new.


Judging the deployability of a protocol change based on whether IETF
participants are able to do so and willing to invest the necessary effort
skews the sample badly. If it were left to us we would have been using IPv6
for over a decade already.



On Thu, Nov 1, 2012 at 12:38 PM, Lucy Lynch <llynch@civil-tongue.net> wrote:

> On Thu, 1 Nov 2012, Phillip Hallam-Baker wrote:
>
>  This is about barely capable sysadmins.
>>
>
> I'm a barely capable sysadmin and the steps Ben outlined seem both
> reasonable and do-able to me. I also like the option to build it into the
> server where smart hands can build it into the default options for
> configuration -
>
> - Lucy
>
>
>  Different problem.
>>
>>
>> On Thu, Nov 1, 2012 at 11:14 AM, Paul Hoffman <paul.hoffman@vpnc.org>
>> wrote:
>>
>>  On Nov 1, 2012, at 2:10 AM, Ben Laurie <benl@google.com> wrote:
>>>
>>>  Its only software. The process of participating in CT for a server
>>>>
>>> operator is:
>>>
>>>>
>>>> 1. Run command line tool once, giving it your certificate as input and
>>>> an SCT file as output.
>>>>
>>>> 2. Add one line of configuration to your server config.
>>>>
>>>> Not exactly rocket science. If people _really_ find it hard, we could
>>>> build it into the servers so there was no manual step at all.
>>>>
>>>
>>> As someone who has to trust every CA in the root pile in my browsers and
>>> OSs, I find it frightening that a CA who can say "this is your bank's
>>> certificate" cannot handle new requirements for how to say that. If
>>> adopting a simple protocol like this causes an ossified CA too many
>>> problems, maybe I don't trust that CA to be able to issue certificates
>>> for
>>> my bank, much less to be able to know which certificates that they are
>>> actually issuing.
>>>
>>> --Paul Hoffman
>>> ______________________________**_________________
>>> therightkey mailing list
>>> therightkey@ietf.org
>>> https://www.ietf.org/mailman/**listinfo/therightkey<https://www.ietf.org/mailman/listinfo/therightkey>
>>>
>>>
>>
>>
>>
> _______________________________________________
> therightkey mailing list
> therightkey@ietf.org
> https://www.ietf.org/mailman/listinfo/therightkey
>
>


-- 
Website: http://hallambaker.com/

--e89a8fb20592e4b95604cd7243d5
Content-Type: text/html; charset=ISO-8859-1
Content-Transfer-Encoding: quoted-printable

>From my perspective it is much cheaper for me to build a tool that does the=
 job right and give it to you than to follow the usual approach of yet more=
 poorly designed and documented stuff that might work or might not.<div>
<br></div><div>Having worked in Web security over 20 years now, I have stil=
l to see a case where a system was breached because of a really subtle desi=
gn flaw. Every security issue I have seen has been really simple once it ha=
s been identified and isolated.</div>
<div><br></div><div>Computer systems are hard to run and harder to secure b=
ecause of the volume of complexity rather than the degree of complexity. Ea=
ch individual step is trivial in itself but the cumulative effect is very l=
arge. I am sitting next to the print edition of the Oxford English Dictiona=
ry which is 20 volumes of dense print. It is something like 200Mb in total.=
 That was the pinacle of achievement of Victorian research taking several d=
ecades and thousands of authors. Modern operating systems and applications =
are much larger. And because we design and build them in the wrong way it o=
nly takes one mistake for them to fail.</div>
<div><br></div><div>One way that real world sysops defend themselves agains=
t complexity is to refuse to learn anything that is new.</div><div><br></di=
v><div><br></div><div>Judging the deployability of a protocol change based =
on whether IETF participants are able to do so and willing to invest the ne=
cessary effort skews the sample badly. If it were left to us we would have =
been using IPv6 for over a decade already.</div>
<div><br></div><div class=3D"gmail_extra"><br><br><div class=3D"gmail_quote=
">On Thu, Nov 1, 2012 at 12:38 PM, Lucy Lynch <span dir=3D"ltr">&lt;<a href=
=3D"mailto:llynch@civil-tongue.net" target=3D"_blank">llynch@civil-tongue.n=
et</a>&gt;</span> wrote:<br>
<blockquote class=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1p=
x #ccc solid;padding-left:1ex"><div class=3D"im">On Thu, 1 Nov 2012, Philli=
p Hallam-Baker wrote:<br>
<br>
<blockquote class=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1p=
x #ccc solid;padding-left:1ex">
This is about barely capable sysadmins.<br>
</blockquote>
<br></div>
I&#39;m a barely capable sysadmin and the steps Ben outlined seem both reas=
onable and do-able to me. I also like the option to build it into the serve=
r where smart hands can build it into the default options for configuration=
 -<br>

<br>
- Lucy<div class=3D"HOEnZb"><div class=3D"h5"><br>
<br>
<blockquote class=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1p=
x #ccc solid;padding-left:1ex">
Different problem.<br>
<br>
<br>
On Thu, Nov 1, 2012 at 11:14 AM, Paul Hoffman &lt;<a href=3D"mailto:paul.ho=
ffman@vpnc.org" target=3D"_blank">paul.hoffman@vpnc.org</a>&gt; wrote:<br>
<br>
<blockquote class=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1p=
x #ccc solid;padding-left:1ex">
On Nov 1, 2012, at 2:10 AM, Ben Laurie &lt;<a href=3D"mailto:benl@google.co=
m" target=3D"_blank">benl@google.com</a>&gt; wrote:<br>
<br>
<blockquote class=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1p=
x #ccc solid;padding-left:1ex">
Its only software. The process of participating in CT for a server<br>
</blockquote>
operator is:<br>
<blockquote class=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1p=
x #ccc solid;padding-left:1ex">
<br>
1. Run command line tool once, giving it your certificate as input and<br>
an SCT file as output.<br>
<br>
2. Add one line of configuration to your server config.<br>
<br>
Not exactly rocket science. If people _really_ find it hard, we could<br>
build it into the servers so there was no manual step at all.<br>
</blockquote>
<br>
As someone who has to trust every CA in the root pile in my browsers and<br=
>
OSs, I find it frightening that a CA who can say &quot;this is your bank&#3=
9;s<br>
certificate&quot; cannot handle new requirements for how to say that. If<br=
>
adopting a simple protocol like this causes an ossified CA too many<br>
problems, maybe I don&#39;t trust that CA to be able to issue certificates =
for<br>
my bank, much less to be able to know which certificates that they are<br>
actually issuing.<br>
<br>
--Paul Hoffman<br>
______________________________<u></u>_________________<br>
therightkey mailing list<br>
<a href=3D"mailto:therightkey@ietf.org" target=3D"_blank">therightkey@ietf.=
org</a><br>
<a href=3D"https://www.ietf.org/mailman/listinfo/therightkey" target=3D"_bl=
ank">https://www.ietf.org/mailman/<u></u>listinfo/therightkey</a><br>
<br>
</blockquote>
<br>
<br>
<br>
</blockquote>
</div></div><br>_______________________________________________<br>
therightkey mailing list<br>
<a href=3D"mailto:therightkey@ietf.org">therightkey@ietf.org</a><br>
<a href=3D"https://www.ietf.org/mailman/listinfo/therightkey" target=3D"_bl=
ank">https://www.ietf.org/mailman/listinfo/therightkey</a><br>
<br></blockquote></div><br><br clear=3D"all"><div><br></div>-- <br>Website:=
 <a href=3D"http://hallambaker.com/">http://hallambaker.com/</a><br><br>
</div>

--e89a8fb20592e4b95604cd7243d5--

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Cc: Lucy Lynch <llynch@civil-tongue.net>, "therightkey@ietf.org" <therightkey@ietf.org>, Paul Hoffman <paul.hoffman@vpnc.org>
Subject: Re: [therightkey] Barely-capable CAs
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On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:
> Having worked in Web security over 20 years now, I have still to see a case
> where a system was breached because of a really subtle design flaw. 

Bleichenbacher?

S.

From paul.hoffman@vpnc.org  Thu Nov  1 11:01:42 2012
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To: "therightkey@ietf.org" <therightkey@ietf.org>
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Subject: Re: [therightkey] Barely-capable CAs
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On Nov 1, 2012, at 10:08 AM, Rick Andrews <Rick_Andrews@symantec.com> =
wrote:

>> As someone who has to trust every CA in the root pile in my browsers
>> and OSs, I find it frightening that a CA who can say "this is your
>> bank's certificate" cannot handle new requirements for how to say =
that.
>> If adopting a simple protocol like this causes an ossified CA too =
many
>> problems, maybe I don't trust that CA to be able to issue =
certificates
>> for my bank, much less to be able to know which certificates that =
they
>> are actually issuing.
>=20
> Paul, I find your statements to be oversimplifications:
>=20
> 1) That the CT protocol is simple: I've been trying to make the point =
on this list that it may be conceptually simple but pretty difficult to =
implement to the scale that is required.

Required by whom? Your scale arguments have, I believe, been that we =
need the same number of CAs in the root pile as we do now, and that we =
need dozens of auditors for the relying parties to choose from. For me =
as a relying part, neither of those are true.

If I'm wrong about my interpretation of your scale arguments, by all =
means start a new thread on this list with a concise statement of what =
you think is required for scaling.=20

> 2) That CAs can't handle new requirements:

That's silly: I believe that many CAs can handle the new requirements =
just fine.

> I'm not convinced that CT is the silver bullet that some appear to =
claim it is.

Now you're putting words in other people's mouths, not a great tactic in =
the IETF. The term "silver bullet" has not appeared on this list, and I =
don't remember anyone using anything at all similar when describing =
certificate transparency.

> If you were referring to my statements on this list, please don't =
interpret my criticism as inability to handle new requirements.

I didn't.

> I think a debate on the merits is healthy.

Yes, that's why we are all here.

--Paul Hoffman=

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Date: Thu, 1 Nov 2012 14:13:30 -0400
Message-ID: <CAMm+Lwgn=hLvKkmMmn9r7BExg6P413YNFWp2o0CS9Mx6NLDv7g@mail.gmail.com>
From: Phillip Hallam-Baker <hallam@gmail.com>
To: Stephen Farrell <stephen.farrell@cs.tcd.ie>
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Cc: Lucy Lynch <llynch@civil-tongue.net>, "therightkey@ietf.org" <therightkey@ietf.org>, Paul Hoffman <paul.hoffman@vpnc.org>
Subject: Re: [therightkey] Barely-capable CAs
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Which depended on a subtle mistake in the SSL 3.0 protocol. Specifically,
it gave a different report depending on whether the text decrypted or not.

Rather ironically here, the specific flaw in SSL 3.0 that made the attack
possible was one that the designer of 3.0 had actually played a major part
in raising in the civil field. Paul Kocher's other work being exploiting
differences in the physical behavior of devices running crypto (timing,
behavior in fault situation, radiation).

Now if Netscape had not been so chronically mismanaged as to only allow
Paul two weeks to review the spec and to only give Knight 10 days to write
Javascript, well the history of Web Security might have been rather
different.




On Thu, Nov 1, 2012 at 2:00 PM, Stephen Farrell
<stephen.farrell@cs.tcd.ie>wrote:

>
>
> On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:
> > Having worked in Web security over 20 years now, I have still to see a
> case
> > where a system was breached because of a really subtle design flaw.
>
> Bleichenbacher?
>
> S.
>



-- 
Website: http://hallambaker.com/

--14dae93a113df26af104cd72f953
Content-Type: text/html; charset=ISO-8859-1
Content-Transfer-Encoding: quoted-printable

Which depended on a subtle mistake in the SSL 3.0 protocol. Specifically, i=
t gave a different report depending on whether the text decrypted or not.<d=
iv><br></div><div>Rather ironically here, the specific flaw in SSL 3.0 that=
 made the attack possible was one that the designer of 3.0 had actually pla=
yed a major part in raising in the civil field. Paul Kocher&#39;s other wor=
k being exploiting differences in the physical behavior of devices running =
crypto (timing, behavior in fault situation, radiation).</div>
<div><br></div><div>Now if Netscape had not been so chronically mismanaged =
as to only allow Paul two weeks to review the spec and to only give Knight =
10 days to write Javascript, well the history of Web Security might have be=
en rather different.</div>
<div><br></div><div><br></div><div class=3D"gmail_extra"><br><br><div class=
=3D"gmail_quote">On Thu, Nov 1, 2012 at 2:00 PM, Stephen Farrell <span dir=
=3D"ltr">&lt;<a href=3D"mailto:stephen.farrell@cs.tcd.ie" target=3D"_blank"=
>stephen.farrell@cs.tcd.ie</a>&gt;</span> wrote:<br>
<blockquote class=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1p=
x #ccc solid;padding-left:1ex"><div class=3D"im"><br>
<br>
On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:<br>
&gt; Having worked in Web security over 20 years now, I have still to see a=
 case<br>
&gt; where a system was breached because of a really subtle design flaw.<br=
>
<br>
</div>Bleichenbacher?<br>
<span class=3D"HOEnZb"><font color=3D"#888888"><br>
S.<br>
</font></span></blockquote></div><br><br clear=3D"all"><div><br></div>-- <b=
r>Website: <a href=3D"http://hallambaker.com/">http://hallambaker.com/</a><=
br><br>
</div>

--14dae93a113df26af104cd72f953--

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Date: Thu, 1 Nov 2012 18:35:11 +0000
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Subject: Re: [therightkey] Barely-capable CAs
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On 1 November 2012 18:00, Stephen Farrell <stephen.farrell@cs.tcd.ie> wrote:
>
>
> On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:
>> Having worked in Web security over 20 years now, I have still to see a case
>> where a system was breached because of a really subtle design flaw.
>
> Bleichenbacher?

TLS renegotiation?

>
> S.
> _______________________________________________
> therightkey mailing list
> therightkey@ietf.org
> https://www.ietf.org/mailman/listinfo/therightkey

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From: Phillip Hallam-Baker <hallam@gmail.com>
To: Ben Laurie <benl@google.com>
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Cc: Lucy Lynch <llynch@civil-tongue.net>, Paul Hoffman <paul.hoffman@vpnc.org>, "therightkey@ietf.org" <therightkey@ietf.org>, Stephen Farrell <stephen.farrell@cs.tcd.ie>
Subject: Re: [therightkey] Barely-capable CAs
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Again, does it appear so subtle after it has been discovered?

Would the flaw have been discovered sooner if there was not so much dead
code?


On Thu, Nov 1, 2012 at 2:35 PM, Ben Laurie <benl@google.com> wrote:

> On 1 November 2012 18:00, Stephen Farrell <stephen.farrell@cs.tcd.ie>
> wrote:
> >
> >
> > On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:
> >> Having worked in Web security over 20 years now, I have still to see a
> case
> >> where a system was breached because of a really subtle design flaw.
> >
> > Bleichenbacher?
>
> TLS renegotiation?
>
> >
> > S.
> > _______________________________________________
> > therightkey mailing list
> > therightkey@ietf.org
> > https://www.ietf.org/mailman/listinfo/therightkey
>



-- 
Website: http://hallambaker.com/

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Again, does it appear so subtle after it has been discovered?<div><br></div><div>Would the flaw have been discovered sooner if there was not so much dead code?</div><div class="gmail_extra"><br><br><div class="gmail_quote">
On Thu, Nov 1, 2012 at 2:35 PM, Ben Laurie <span dir="ltr">&lt;<a href="mailto:benl@google.com" target="_blank">benl@google.com</a>&gt;</span> wrote:<br><blockquote class="gmail_quote" style="margin:0 0 0 .8ex;border-left:1px #ccc solid;padding-left:1ex">
<div class="HOEnZb"><div class="h5">On 1 November 2012 18:00, Stephen Farrell &lt;<a href="mailto:stephen.farrell@cs.tcd.ie">stephen.farrell@cs.tcd.ie</a>&gt; wrote:<br>
&gt;<br>
&gt;<br>
&gt; On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:<br>
&gt;&gt; Having worked in Web security over 20 years now, I have still to see a case<br>
&gt;&gt; where a system was breached because of a really subtle design flaw.<br>
&gt;<br>
&gt; Bleichenbacher?<br>
<br>
</div></div>TLS renegotiation?<br>
<br>
&gt;<br>
&gt; S.<br>
<div class="HOEnZb"><div class="h5">&gt; _______________________________________________<br>
&gt; therightkey mailing list<br>
&gt; <a href="mailto:therightkey@ietf.org">therightkey@ietf.org</a><br>
&gt; <a href="https://www.ietf.org/mailman/listinfo/therightkey" target="_blank">https://www.ietf.org/mailman/listinfo/therightkey</a><br>
</div></div></blockquote></div><br><br clear="all"><div><br></div>-- <br>Website: <a href="http://hallambaker.com/">http://hallambaker.com/</a><br><br>
</div>

--e89a8fb1f72c5db5b304cd735486--

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Cc: "therightkey@ietf.org" <therightkey@ietf.org>
Subject: Re: [therightkey] Barely-capable CAs
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On 01/11/12 16:46, Paul Hoffman wrote:
> On Nov 1, 2012, at 9:29 AM, Phillip Hallam-Baker <hallam@gmail.com> wrote:
>
>> This is about barely capable sysadmins.
>>
>> Different problem.
>
>>From the perspective of the relying party (me, caring about making a secure connection to my bank), the problems are indistinguishable. A CA who retains a sysadmin who is barely capable

Paul, this is about barely capable sysadmins _at your bank_, not at the CA.

(Ben wrote "The process of participating in CT for a _server operator_ 
is...")

> deserves less trust than one who retains sysadmins who are capable.

Obviously I agree that CAs should retain capable sysadmins.

-- 
Rob Stradling
Senior Research & Development Scientist
COMODO - Creating Trust Online

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From: Nico Williams <nico@cryptonector.com>
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Subject: Re: [therightkey] Barely-capable CAs
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On Thu, Nov 1, 2012 at 11:29 AM, Phillip Hallam-Baker <hallam@gmail.com> wrote:
> This is about barely capable sysadmins.

And the barely capable management that fails to make up for barely
capable sysadmins by, e.g., hiring actually capable sysadmins or
engaging consultants to help with occasional operations changes like
CT.

Nico
--

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From: Ben Laurie <benl@google.com>
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Subject: Re: [therightkey] Barely-capable CAs
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On 1 November 2012 18:38, Phillip Hallam-Baker <hallam@gmail.com> wrote:
> Again, does it appear so subtle after it has been discovered?

Well, I find I have to remind myself how it works. So ... yeah.

Also, I assumed Bliechanbacher was the exponent 3 thing, which was
also pretty subtle.

>
> Would the flaw have been discovered sooner if there was not so much dead
> code?

I don't think dead code had any influence on either of these.

>
>
> On Thu, Nov 1, 2012 at 2:35 PM, Ben Laurie <benl@google.com> wrote:
>>
>> On 1 November 2012 18:00, Stephen Farrell <stephen.farrell@cs.tcd.ie>
>> wrote:
>> >
>> >
>> > On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:
>> >> Having worked in Web security over 20 years now, I have still to see a
>> >> case
>> >> where a system was breached because of a really subtle design flaw.
>> >
>> > Bleichenbacher?
>>
>> TLS renegotiation?
>>
>> >
>> > S.
>> > _______________________________________________
>> > therightkey mailing list
>> > therightkey@ietf.org
>> > https://www.ietf.org/mailman/listinfo/therightkey
>
>
>
>
> --
> Website: http://hallambaker.com/
>

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To: Rob Stradling <rob.stradling@comodo.com>
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Subject: Re: [therightkey] Barely-capable CAs
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On Nov 1, 2012, at 11:52 AM, Rob Stradling <rob.stradling@comodo.com> =
wrote:

> On 01/11/12 16:46, Paul Hoffman wrote:
>> On Nov 1, 2012, at 9:29 AM, Phillip Hallam-Baker <hallam@gmail.com> =
wrote:
>>=20
>>> This is about barely capable sysadmins.
>>>=20
>>> Different problem.
>>=20
>>> =46rom the perspective of the relying party (me, caring about making =
a secure connection to my bank), the problems are indistinguishable. A =
CA who retains a sysadmin who is barely capable
>=20
> Paul, this is about barely capable sysadmins _at your bank_, not at =
the CA.
>=20
> (Ben wrote "The process of participating in CT for a _server operator_ =
is...")

OK, maybe I'm confused here, or maybe you are. If my bank has a =
certificate issued by a CA who is actively participating in CT, there is =
no requirement on the bank at all, correct?

--Paul Hoffman=

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Cc: therightkey@ietf.org
Subject: Re: [therightkey] Barely-capable CAs
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On 01/11/12 19:54, Paul Hoffman wrote:
> On Nov 1, 2012, at 11:52 AM, Rob Stradling <rob.stradling@comodo.com> wrote:
>
>> On 01/11/12 16:46, Paul Hoffman wrote:
>>> On Nov 1, 2012, at 9:29 AM, Phillip Hallam-Baker <hallam@gmail.com> wrote:
>>>
>>>> This is about barely capable sysadmins.
>>>>
>>>> Different problem.
>>>
>>>>  From the perspective of the relying party (me, caring about making a secure connection to my bank), the problems are indistinguishable. A CA who retains a sysadmin who is barely capable
>>
>> Paul, this is about barely capable sysadmins _at your bank_, not at the CA.
>>
>> (Ben wrote "The process of participating in CT for a _server operator_ is...")
>
> OK, maybe I'm confused here, or maybe you are. If my bank has a certificate issued by a CA who is actively participating in CT, there is no requirement on the bank at all, correct?

If by "actively participating" you mean that the CA has embedded the CT 
proof in the cert, then yes, there is no requirement on the bank.

If the CA instead embeds the CT proof in OCSP Responses relating to the 
cert, then there is no requirement on the bank apart from to use OCSP 
Stapling.

If the CA is not participating in either of these 2 ways, then there is 
a requirement on the bank (aka the "server operator"), which may or may 
not be rocket science, depending on your opinion.

-- 
Rob Stradling
Senior Research & Development Scientist
COMODO - Creating Trust Online

From hallam@gmail.com  Thu Nov  1 13:01:04 2012
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Date: Thu, 1 Nov 2012 16:01:03 -0400
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From: Phillip Hallam-Baker <hallam@gmail.com>
To: Ben Laurie <benl@google.com>
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Cc: Lucy Lynch <llynch@civil-tongue.net>, Paul Hoffman <paul.hoffman@vpnc.org>, "therightkey@ietf.org" <therightkey@ietf.org>, Stephen Farrell <stephen.farrell@cs.tcd.ie>
Subject: Re: [therightkey] Barely-capable CAs
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--14dae9c099b891e50304cd747a60
Content-Type: text/plain; charset=ISO-8859-1

OK so some examples do exist. But really what proportion of real world
compromises do not involve something bone headed like using a 512 bit key
for DKIM signatures?

What I am saying here is not 'don't do CT', I am saying that we have to
make the ease of administration a high priority in the design.


On Thu, Nov 1, 2012 at 3:52 PM, Ben Laurie <benl@google.com> wrote:

> On 1 November 2012 18:38, Phillip Hallam-Baker <hallam@gmail.com> wrote:
> > Again, does it appear so subtle after it has been discovered?
>
> Well, I find I have to remind myself how it works. So ... yeah.
>
> Also, I assumed Bliechanbacher was the exponent 3 thing, which was
> also pretty subtle.
>
> >
> > Would the flaw have been discovered sooner if there was not so much dead
> > code?
>
> I don't think dead code had any influence on either of these.
>
> >
> >
> > On Thu, Nov 1, 2012 at 2:35 PM, Ben Laurie <benl@google.com> wrote:
> >>
> >> On 1 November 2012 18:00, Stephen Farrell <stephen.farrell@cs.tcd.ie>
> >> wrote:
> >> >
> >> >
> >> > On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:
> >> >> Having worked in Web security over 20 years now, I have still to see
> a
> >> >> case
> >> >> where a system was breached because of a really subtle design flaw.
> >> >
> >> > Bleichenbacher?
> >>
> >> TLS renegotiation?
> >>
> >> >
> >> > S.
> >> > _______________________________________________
> >> > therightkey mailing list
> >> > therightkey@ietf.org
> >> > https://www.ietf.org/mailman/listinfo/therightkey
> >
> >
> >
> >
> > --
> > Website: http://hallambaker.com/
> >
>



-- 
Website: http://hallambaker.com/

--14dae9c099b891e50304cd747a60
Content-Type: text/html; charset=ISO-8859-1
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OK so some examples do exist. But really what proportion of real world comp=
romises do not involve something bone headed like using a 512 bit key for D=
KIM signatures?<div><br></div><div>What I am saying here is not &#39;don&#3=
9;t do CT&#39;, I am saying that we have to make the ease of administration=
 a high priority in the design.</div>
<div class=3D"gmail_extra"><br><br><div class=3D"gmail_quote">On Thu, Nov 1=
, 2012 at 3:52 PM, Ben Laurie <span dir=3D"ltr">&lt;<a href=3D"mailto:benl@=
google.com" target=3D"_blank">benl@google.com</a>&gt;</span> wrote:<br><blo=
ckquote class=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1px #c=
cc solid;padding-left:1ex">
<div class=3D"im">On 1 November 2012 18:38, Phillip Hallam-Baker &lt;<a hre=
f=3D"mailto:hallam@gmail.com">hallam@gmail.com</a>&gt; wrote:<br>
&gt; Again, does it appear so subtle after it has been discovered?<br>
<br>
</div>Well, I find I have to remind myself how it works. So ... yeah.<br>
<br>
Also, I assumed Bliechanbacher was the exponent 3 thing, which was<br>
also pretty subtle.<br>
<div class=3D"im"><br>
&gt;<br>
&gt; Would the flaw have been discovered sooner if there was not so much de=
ad<br>
&gt; code?<br>
<br>
</div>I don&#39;t think dead code had any influence on either of these.<br>
<div class=3D"HOEnZb"><div class=3D"h5"><br>
&gt;<br>
&gt;<br>
&gt; On Thu, Nov 1, 2012 at 2:35 PM, Ben Laurie &lt;<a href=3D"mailto:benl@=
google.com">benl@google.com</a>&gt; wrote:<br>
&gt;&gt;<br>
&gt;&gt; On 1 November 2012 18:00, Stephen Farrell &lt;<a href=3D"mailto:st=
ephen.farrell@cs.tcd.ie">stephen.farrell@cs.tcd.ie</a>&gt;<br>
&gt;&gt; wrote:<br>
&gt;&gt; &gt;<br>
&gt;&gt; &gt;<br>
&gt;&gt; &gt; On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:<br>
&gt;&gt; &gt;&gt; Having worked in Web security over 20 years now, I have s=
till to see a<br>
&gt;&gt; &gt;&gt; case<br>
&gt;&gt; &gt;&gt; where a system was breached because of a really subtle de=
sign flaw.<br>
&gt;&gt; &gt;<br>
&gt;&gt; &gt; Bleichenbacher?<br>
&gt;&gt;<br>
&gt;&gt; TLS renegotiation?<br>
&gt;&gt;<br>
&gt;&gt; &gt;<br>
&gt;&gt; &gt; S.<br>
&gt;&gt; &gt; _______________________________________________<br>
&gt;&gt; &gt; therightkey mailing list<br>
&gt;&gt; &gt; <a href=3D"mailto:therightkey@ietf.org">therightkey@ietf.org<=
/a><br>
&gt;&gt; &gt; <a href=3D"https://www.ietf.org/mailman/listinfo/therightkey"=
 target=3D"_blank">https://www.ietf.org/mailman/listinfo/therightkey</a><br=
>
&gt;<br>
&gt;<br>
&gt;<br>
&gt;<br>
&gt; --<br>
&gt; Website: <a href=3D"http://hallambaker.com/" target=3D"_blank">http://=
hallambaker.com/</a><br>
&gt;<br>
</div></div></blockquote></div><br><br clear=3D"all"><div><br></div>-- <br>=
Website: <a href=3D"http://hallambaker.com/">http://hallambaker.com/</a><br=
><br>
</div>

--14dae9c099b891e50304cd747a60--

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References: <7500672F-5BDE-4EBE-ABC3-1AFEF2972D95@vpnc.org> <508A48C5.9070005@comodo.com> <544B0DD62A64C1448B2DA253C0114146069D76E5FC@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM> <CABrd9STHtw__Wm30Z5T27mx8PMb-mScCSa-EZVDdeQvy_Rru1Q@mail.gmail.com> <544B0DD62A64C1448B2DA253C0114146069F66F830@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM> <CABrd9SSJWm_8BY9uN4D6=LmogwkNeLMZtJaOX2MQU1QuCHJwyg@mail.gmail.com> <80A8F0DC-C894-4299-AEC7-12B84A803E84@vpnc.org> <CAMm+Lwh2Qhv8eHtmy=KisShdJiLYe=ziyfezQELqqfu8y9H5qg@mail.gmail.com> <alpine.BSF.2.00.1211010935330.60568@hiroshima.bogus.com> <CAMm+LwjQiJ3aWpAYdy1hxtf09Sf=4g9AO=r-PihSPVkc8PMLkg@mail.gmail.com> <5092B8C4.3070607@cs.tcd.ie> <CABrd9SRKuo-VW6AHapz0NogKSGmcXXtRomTh1bvZudaB5q-GTQ@mail.gmail.com> <CAMm+LwhxLYhEJ213AmvTo6cCfPRq_0X1hxJx1vN13nfxkBWLiw@mail.gmail.com> <CABrd9ST3=4b73jDZb=Cxq6L_+2z7ExCKcY-ywBiD5hW98uAWBw@mail.gmail.com> <CAMm+Lwh3KeAXibf+vE9KW+JJ7XaUSDMkstcTp-LDwCQe7QX8Mg@mail.gmail.com>
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Subject: Re: [therightkey] Barely-capable CAs
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On 01/11/12 20:01, Phillip Hallam-Baker wrote:
> OK so some examples do exist. But really what proportion of real world
> compromises do not involve something bone headed like using a 512 bit
> key for DKIM signatures?
>
> What I am saying here is not 'don't do CT', I am saying that we have to
> make the ease of administration a high priority in the design.

I would say that "ease of administration" for server operators is one of 
the main reasons why Ben is interested in getting CAs to participate!  ;-)

> On Thu, Nov 1, 2012 at 3:52 PM, Ben Laurie <benl@google.com
> <mailto:benl@google.com>> wrote:
>
>     On 1 November 2012 18:38, Phillip Hallam-Baker <hallam@gmail.com
>     <mailto:hallam@gmail.com>> wrote:
>      > Again, does it appear so subtle after it has been discovered?
>
>     Well, I find I have to remind myself how it works. So ... yeah.
>
>     Also, I assumed Bliechanbacher was the exponent 3 thing, which was
>     also pretty subtle.
>
>      >
>      > Would the flaw have been discovered sooner if there was not so
>     much dead
>      > code?
>
>     I don't think dead code had any influence on either of these.
>
>      >
>      >
>      > On Thu, Nov 1, 2012 at 2:35 PM, Ben Laurie <benl@google.com
>     <mailto:benl@google.com>> wrote:
>      >>
>      >> On 1 November 2012 18:00, Stephen Farrell
>     <stephen.farrell@cs.tcd.ie <mailto:stephen.farrell@cs.tcd.ie>>
>      >> wrote:
>      >> >
>      >> >
>      >> > On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:
>      >> >> Having worked in Web security over 20 years now, I have still
>     to see a
>      >> >> case
>      >> >> where a system was breached because of a really subtle design
>     flaw.
>      >> >
>      >> > Bleichenbacher?
>      >>
>      >> TLS renegotiation?
>      >>
>      >> >
>      >> > S.
>      >> > _______________________________________________
>      >> > therightkey mailing list
>      >> > therightkey@ietf.org <mailto:therightkey@ietf.org>
>      >> > https://www.ietf.org/mailman/listinfo/therightkey
>      >
>      >
>      >
>      >
>      > --
>      > Website: http://hallambaker.com/
>      >
>
>
>
>
> --
> Website: http://hallambaker.com/
>
>
>
> _______________________________________________
> therightkey mailing list
> therightkey@ietf.org
> https://www.ietf.org/mailman/listinfo/therightkey
>

-- 
Rob Stradling
Senior Research & Development Scientist
COMODO - Creating Trust Online
Office Tel: +44.(0)1274.730505
Office Fax: +44.(0)1274.730909
www.comodo.com

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To: Phillip Hallam-Baker <hallam@gmail.com>
References: <7500672F-5BDE-4EBE-ABC3-1AFEF2972D95@vpnc.org> <508A48C5.9070005@comodo.com> <544B0DD62A64C1448B2DA253C0114146069D76E5FC@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM> <CABrd9STHtw__Wm30Z5T27mx8PMb-mScCSa-EZVDdeQvy_Rru1Q@mail.gmail.com> <544B0DD62A64C1448B2DA253C0114146069F66F830@TUS1XCHEVSPIN33.SYMC.SYMANTEC.COM> <CABrd9SSJWm_8BY9uN4D6=LmogwkNeLMZtJaOX2MQU1QuCHJwyg@mail.gmail.com> <80A8F0DC-C894-4299-AEC7-12B84A803E84@vpnc.org> <CAMm+Lwh2Qhv8eHtmy=KisShdJiLYe=ziyfezQELqqfu8y9H5qg@mail.gmail.com> <alpine.BSF.2.00.1211010935330.60568@hiroshima.bogus.com> <CAMm+LwjQiJ3aWpAYdy1hxtf09Sf=4g9AO=r-PihSPVkc8PMLkg@mail.gmail.com> <5092B8C4.3070607@cs.tcd.ie> <CABrd9SRKuo-VW6AHapz0NogKSGmcXXtRomTh1bvZudaB5q-GTQ@mail.gmail.com> <CAMm+LwhxLYhEJ213AmvTo6cCfPRq_0X1hxJx1vN13nfxkBWLiw@mail.gmail.com> <CABrd9ST3=4b73jDZb=Cxq6L_+2z7ExCKcY-ywBiD5hW98uAWBw@mail.gmail.com> <CAMm+Lwh3KeAXibf+vE9KW+JJ7XaUSDMkstcTp-LDwCQe7QX8Mg@mail.gmail.com> <5092D644.5020909@comodo.com>
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Cc: "therightkey@ietf.org" <therightkey@ietf.org>, Lucy Lynch <llynch@civil-tongue.net>, Ben Laurie <benl@google.com>, Paul Hoffman <paul.hoffman@vpnc.org>, Stephen Farrell <stephen.farrell@cs.tcd.ie>
Subject: Re: [therightkey] Barely-capable CAs
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On 01/11/12 20:06, Rob Stradling wrote:
> On 01/11/12 20:01, Phillip Hallam-Baker wrote:
>> OK so some examples do exist. But really what proportion of real world
>> compromises do not involve something bone headed like using a 512 bit
>> key for DKIM signatures?
>>
>> What I am saying here is not 'don't do CT', I am saying that we have to
>> make the ease of administration a high priority in the design.
>
> I would say that "ease of administration" for server operators is one of
> the main reasons why Ben is interested in getting CAs to participate!  ;-)

I'm not saying that CA participation in CT will magically make 
administration easy.  ;-)

I am suggesting that having no extra steps to perform is probably 
_easier_ than having some extra steps to perform.

>> On Thu, Nov 1, 2012 at 3:52 PM, Ben Laurie <benl@google.com
>> <mailto:benl@google.com>> wrote:
>>
>>     On 1 November 2012 18:38, Phillip Hallam-Baker <hallam@gmail.com
>>     <mailto:hallam@gmail.com>> wrote:
>>      > Again, does it appear so subtle after it has been discovered?
>>
>>     Well, I find I have to remind myself how it works. So ... yeah.
>>
>>     Also, I assumed Bliechanbacher was the exponent 3 thing, which was
>>     also pretty subtle.
>>
>>      >
>>      > Would the flaw have been discovered sooner if there was not so
>>     much dead
>>      > code?
>>
>>     I don't think dead code had any influence on either of these.
>>
>>      >
>>      >
>>      > On Thu, Nov 1, 2012 at 2:35 PM, Ben Laurie <benl@google.com
>>     <mailto:benl@google.com>> wrote:
>>      >>
>>      >> On 1 November 2012 18:00, Stephen Farrell
>>     <stephen.farrell@cs.tcd.ie <mailto:stephen.farrell@cs.tcd.ie>>
>>      >> wrote:
>>      >> >
>>      >> >
>>      >> > On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:
>>      >> >> Having worked in Web security over 20 years now, I have still
>>     to see a
>>      >> >> case
>>      >> >> where a system was breached because of a really subtle design
>>     flaw.
>>      >> >
>>      >> > Bleichenbacher?
>>      >>
>>      >> TLS renegotiation?
>>      >>
>>      >> >
>>      >> > S.
>>      >> > _______________________________________________
>>      >> > therightkey mailing list
>>      >> > therightkey@ietf.org <mailto:therightkey@ietf.org>
>>      >> > https://www.ietf.org/mailman/listinfo/therightkey
>>      >
>>      >
>>      >
>>      >
>>      > --
>>      > Website: http://hallambaker.com/
>>      >
>>
>>
>>
>>
>> --
>> Website: http://hallambaker.com/
>>
>>
>>
>> _______________________________________________
>> therightkey mailing list
>> therightkey@ietf.org
>> https://www.ietf.org/mailman/listinfo/therightkey
>>
>

-- 
Rob Stradling
Senior Research & Development Scientist
COMODO - Creating Trust Online
Office Tel: +44.(0)1274.730505
Office Fax: +44.(0)1274.730909
www.comodo.com

COMODO CA Limited, Registered in England No. 04058690
Registered Office:
   3rd Floor, 26 Office Village, Exchange Quay,
   Trafford Road, Salford, Manchester M5 3EQ

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From paul.hoffman@vpnc.org  Thu Nov  1 13:34:03 2012
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To: "therightkey@ietf.org" <therightkey@ietf.org>
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Subject: Re: [therightkey] Barely-capable CAs
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On Nov 1, 2012, at 1:00 PM, Rob Stradling <rob.stradling@comodo.com> =
wrote:

> If by "actively participating" you mean that the CA has embedded the =
CT proof in the cert, then yes, there is no requirement on the bank.

That's one definition of "actively participating", but there are others, =
such as publishing a list that the auditors pick up.

> If the CA instead embeds the CT proof in OCSP Responses relating to =
the cert, then there is no requirement on the bank apart from to use =
OCSP Stapling.

This confuses me. If the CA is putting the CT proof in its OCSP =
responses, why does the bank have to do anything?

> If the CA is not participating in either of these 2 ways, then there =
is a requirement on the bank (aka the "server operator"), which may or =
may not be rocket science, depending on your opinion.

If the CA is not participating, why should that CA be in the trust pile =
of software that relies on CT?

--Paul Hoffman=

From rob.stradling@comodo.com  Thu Nov  1 14:55:59 2012
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Cc: "therightkey@ietf.org" <therightkey@ietf.org>
Subject: Re: [therightkey] Barely-capable CAs
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On 01/11/12 20:33, Paul Hoffman wrote:
> On Nov 1, 2012, at 1:00 PM, Rob Stradling <rob.stradling@comodo.com> wrote:
>
>> If by "actively participating" you mean that the CA has embedded the CT proof in the cert, then yes, there is no requirement on the bank.
>
> That's one definition of "actively participating", but there are others, such as publishing a list that the auditors pick up.

What sort of list did you have in mind?

Would this list be "transparent"?
(i.e. if the CA were to publish an inaccurate or incomplete list, would 
the auditor definitely notice?)

>> If the CA instead embeds the CT proof in OCSP Responses relating to the cert, then there is no requirement on the bank apart from to use OCSP Stapling.
>
> This confuses me. If the CA is putting the CT proof in its OCSP responses, why does the bank have to do anything?

Because not all clients do online OCSP checks.
Because far too many online OCSP checks fail due to the Responder being 
unreachable.
Because OCSP Stapling is not currently enabled by default in (at least) 
Apache and nginx.

>> If the CA is not participating in either of these 2 ways, then there is a requirement on the bank (aka the "server operator"), which may or may not be rocket science, depending on your opinion.
>
> If the CA is not participating, why should that CA be in the trust pile of software that relies on CT?

AFAIK, this is the first time it's been suggested that CT should require 
CA participation.  I think it's an idea we should consider seriously.

-- 
Rob Stradling
Senior Research & Development Scientist
COMODO - Creating Trust Online

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Cc: "therightkey@ietf.org" <therightkey@ietf.org>
Subject: Re: [therightkey] Barely-capable CAs
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On 01/11/12 21:55, Rob Stradling wrote:
> On 01/11/12 20:33, Paul Hoffman wrote:
>> On Nov 1, 2012, at 1:00 PM, Rob Stradling <rob.stradling@comodo.com>
>> wrote:
>>
>>> If by "actively participating" you mean that the CA has embedded the
>>> CT proof in the cert, then yes, there is no requirement on the bank.
>>
>> That's one definition of "actively participating", but there are
>> others, such as publishing a list that the auditors pick up.
>
> What sort of list did you have in mind?
 >
 > Would this list be "transparent"?
 > (i.e. if the CA were to publish an inaccurate or incomplete list,
 > would the auditor definitely notice?)

Ah, perhaps you've got this agenda item in mind:

"JSON format for CAs to report recent certificate
issuance, Phill Hallam-Baker – 10 mins"

I think Phill coined the term "weak transparency" for this sort of 
thing.  I'd only been thinking about Ben's "strong transparency" 
sunlight-02 proposal in this thread so far.

<snip>

-- 
Rob Stradling
Senior Research & Development Scientist
COMODO - Creating Trust Online

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Subject: Re: [therightkey] Barely-capable CAs
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Stephen Farrell wrote:
> 
> 
> On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:
> > Having worked in Web security over 20 years now, I have still to see a case
> > where a system was breached because of a really subtle design flaw. 
> 
> Bleichenbacher?

Debian OpenSSL CPRNG goof?

-Martin

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Subject: Re: [therightkey] Barely-capable CAs
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On Nov 1, 2012, at 11:00 AM, Stephen Farrell <stephen.farrell@cs.tcd.ie> =
wrote:

>=20
>=20
> On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:
>> Having worked in Web security over 20 years now, I have still to see =
a case
>> where a system was breached because of a really subtle design flaw.=20=

>=20
> Bleichenbacher?

Maybe. By the time Bleichenbacher was actually an issue, a number of us =
had been screaming for years. I suppose you can say that it was really =
subtle because the people concerned about it weren't listened to. But =
that has its own ick factor, too. Everything that people don't believe =
is subtle. Is it subtle that you shouldn't be using 1024 bit RSA keys? =
512?

	Jon


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Subject: Re: [therightkey] Barely-capable CAs
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On Nov 1, 2012, at 8:14 AM, Paul Hoffman <paul.hoffman@vpnc.org> wrote:

> As someone who has to trust every CA in the root pile in my browsers =
and OSs, I find it frightening that a CA who can say "this is your =
bank's certificate" cannot handle new requirements for how to say that. =
If adopting a simple protocol like this causes an ossified CA too many =
problems, maybe I don't trust that CA to be able to issue certificates =
for my bank, much less to be able to know which certificates that they =
are actually issuing.

I'm mostly with Paul on this. I think that a CA that doesn't see CT as =
an incredible boon to be ossified to say the least. I'd add that this =
can be something the market solves -- move your business to one that =
gets it.

I can't say enough good things about CT because I think it lets everyone =
win without being the TSA of the Internet. I can go on, but really, CT =
is almost all upside. The only real downside is that it puts stresses on =
genuinely private PKIs, but it's only a stress, and arguably the few of =
those that really exist can opt out. Ben has pointed out that the same =
sorts of problems that CT would put on such things are induced by the =
SSL Observatory and similar efforts.

	Jon


From hallam@gmail.com  Fri Nov  2 19:10:57 2012
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Date: Fri, 2 Nov 2012 22:10:56 -0400
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From: Phillip Hallam-Baker <hallam@gmail.com>
To: Jon Callas <jon@callas.org>
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Cc: "therightkey@ietf.org" <therightkey@ietf.org>
Subject: Re: [therightkey] Barely-capable CAs
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--14dae93b63203c44a104cd8dc313
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My original point was that adding additional complexity into the system is
never simple. It is not just the small increment of complexity added that
is the issue, it is how it interacts with all the existing increments of
complexity.

Network admin is very hard because the tools provided are total crap. It
would be very easy for parts of the network to give feedback such as 'which
port is hogging bandwidth by jabbering away in NETBIOS' but they don't.

Net admins tend to be very suspicious of changes to configurations for good
reason, they have been burned many times before by 'simple' changes.

As for people warning about bugs... well yes, I told netscape about the
flaw in their PRNG over a year before someone decompiled the code and
'discovered' it. Jeff Schiller and Alan Schiffman had both been on at me
about the pitfalls of RNGs. Jeff because the Kerberos people got burned
that way.


What it comes down to in part is that some of us have a very different
model of how to write code than the rest of you. Cross site scripting, SQL
injection, buffer overruns, simply cannot occur in my coding world because
I would never use a scripting language that way or SQL or have code without
pervasive bound checking.

The NSA avoids errors like Bleichenbacher in the same way. Perhaps we can
learn from them.

In the meantime, if we want to get past the net admins we have to give them
a royal road and not lecture them.


On Fri, Nov 2, 2012 at 8:52 PM, Jon Callas <jon@callas.org> wrote:

>
> On Nov 1, 2012, at 11:00 AM, Stephen Farrell <stephen.farrell@cs.tcd.ie>
> wrote:
>
> >
> >
> > On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:
> >> Having worked in Web security over 20 years now, I have still to see a
> case
> >> where a system was breached because of a really subtle design flaw.
> >
> > Bleichenbacher?
>
> Maybe. By the time Bleichenbacher was actually an issue, a number of us
> had been screaming for years. I suppose you can say that it was really
> subtle because the people concerned about it weren't listened to. But that
> has its own ick factor, too. Everything that people don't believe is
> subtle. Is it subtle that you shouldn't be using 1024 bit RSA keys? 512?
>
>         Jon
>
> _______________________________________________
> therightkey mailing list
> therightkey@ietf.org
> https://www.ietf.org/mailman/listinfo/therightkey
>



-- 
Website: http://hallambaker.com/

--14dae93b63203c44a104cd8dc313
Content-Type: text/html; charset=ISO-8859-1
Content-Transfer-Encoding: quoted-printable

My original point was that adding additional complexity into the system is =
never simple. It is not just the small increment of complexity added that i=
s the issue, it is how it interacts with all the existing increments of com=
plexity.<div>
<br></div><div>Network admin is very hard because the tools provided are to=
tal crap. It would be very easy for parts of the network to give feedback s=
uch as &#39;which port is hogging bandwidth by jabbering away in NETBIOS&#3=
9; but they don&#39;t.=A0</div>
<div><br></div><div>Net admins tend to be very suspicious of changes to con=
figurations for good reason, they have been burned many times before by &#3=
9;simple&#39; changes.</div><div><br></div><div>As for people warning about=
 bugs... well yes, I told netscape about the flaw in their PRNG over a year=
 before someone decompiled the code and &#39;discovered&#39; it. Jeff Schil=
ler and Alan Schiffman had both been on at me about the pitfalls of RNGs. J=
eff because the Kerberos people got burned that way.</div>
<div><br></div><div><br></div><div>What it comes down to in part is that so=
me of us have a very different model of how to write code than the rest of =
you. Cross site scripting, SQL injection, buffer overruns, simply cannot oc=
cur in my coding world because I would never use a scripting language that =
way or SQL or have code without pervasive bound checking.</div>
<div><br></div><div>The NSA avoids errors like=A0<span style=3D"font-family=
:arial,sans-serif;font-size:12.800000190734863px">Bleichenbacher in the sam=
e way. Perhaps we can learn from them.</span></div><div><span style=3D"font=
-family:arial,sans-serif;font-size:12.800000190734863px"><br>
</span></div><div><span style=3D"font-family:arial,sans-serif;font-size:12.=
800000190734863px">In the meantime, if we want to get past the net admins w=
e have to give them a royal road and not lecture them.</span></div><div cla=
ss=3D"gmail_extra">
<br><br><div class=3D"gmail_quote">On Fri, Nov 2, 2012 at 8:52 PM, Jon Call=
as <span dir=3D"ltr">&lt;<a href=3D"mailto:jon@callas.org" target=3D"_blank=
">jon@callas.org</a>&gt;</span> wrote:<br><blockquote class=3D"gmail_quote"=
 style=3D"margin:0 0 0 .8ex;border-left:1px #ccc solid;padding-left:1ex">
<div class=3D"HOEnZb"><div class=3D"h5"><br>
On Nov 1, 2012, at 11:00 AM, Stephen Farrell &lt;<a href=3D"mailto:stephen.=
farrell@cs.tcd.ie">stephen.farrell@cs.tcd.ie</a>&gt; wrote:<br>
<br>
&gt;<br>
&gt;<br>
&gt; On 11/01/2012 05:22 PM, Phillip Hallam-Baker wrote:<br>
&gt;&gt; Having worked in Web security over 20 years now, I have still to s=
ee a case<br>
&gt;&gt; where a system was breached because of a really subtle design flaw=
.<br>
&gt;<br>
&gt; Bleichenbacher?<br>
<br>
</div></div>Maybe. By the time Bleichenbacher was actually an issue, a numb=
er of us had been screaming for years. I suppose you can say that it was re=
ally subtle because the people concerned about it weren&#39;t listened to. =
But that has its own ick factor, too. Everything that people don&#39;t beli=
eve is subtle. Is it subtle that you shouldn&#39;t be using 1024 bit RSA ke=
ys? 512?<br>

<span class=3D"HOEnZb"><font color=3D"#888888"><br>
=A0 =A0 =A0 =A0 Jon<br>
</font></span><div class=3D"HOEnZb"><div class=3D"h5"><br>
_______________________________________________<br>
therightkey mailing list<br>
<a href=3D"mailto:therightkey@ietf.org">therightkey@ietf.org</a><br>
<a href=3D"https://www.ietf.org/mailman/listinfo/therightkey" target=3D"_bl=
ank">https://www.ietf.org/mailman/listinfo/therightkey</a><br>
</div></div></blockquote></div><br><br clear=3D"all"><div><br></div>-- <br>=
Website: <a href=3D"http://hallambaker.com/">http://hallambaker.com/</a><br=
><br>
</div>

--14dae93b63203c44a104cd8dc313--

From stephen.farrell@cs.tcd.ie  Tue Nov 13 05:10:13 2012
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Date: Tue, 13 Nov 2012 13:09:35 +0000
From: Stephen Farrell <stephen.farrell@cs.tcd.ie>
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Subject: [therightkey] certrans BoF outcome
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Hi all,

Last week's BoF went very well from my point of
view, so first some thanks...

Thanks to Paul for chairing and to Adam for a
great slide-free presentation and to Phill for
his presentation. (As an aside, few/zero slides
at BoFs like this one seems like a fine plan in
general.) Thanks also to Wes Hardaker for taking
notes, which are posted [1] to the meeting
materials. Let Paul or I know if there are any
changes needed to those. And last but not least
thanks to all who took part in the constructive
and interesting discussion.

In terms of outcome, the way forward is that Ben
will continue working on his sunlight draft to
bring it to the point where he thinks its ready
to be an experimental-track RFC. When he and I are
happy with that, I'll AD sponsor it, which means
it'll get an IETF last call after which it can
go to the IESG for evaluation, all going well.

Around then we can re-visit whether forming a WG
is appropriate, my feeling from last week is that
that may well be the case. If so, we can discuss
then if another BoF or just crafting a charter and
forging ahead is the way to do that.

We can continue to use this list for all that work,
so if you have comments on the sunlight draft [2]
please send those so that Ben can see them and
take them into account.

There's probably a bit of thought needed about
how much to try get done in the experimental
track RFC and I'll chat with Ben about that and
one of us will summarise that to the list so
folks know what to expect when this does pop
out for an IETF LC. I hope we can get that plan
sent to the list in the next week-ish.

There were also some new issues that were raised
at the BoF (see the notes [1]) and more discussion
of those on this list would also be good. (But
do start new threads for those please.)

Regards,
Stephen.

[1] http://www.ietf.org/proceedings/85/minutes/minutes-85-certrans
[2] http://tools.ietf.org/html/draft-laurie-pki-sunlight

From benl@google.com  Wed Nov 14 07:48:23 2012
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Subject: [therightkey] DANE and CT
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At the CT BoF the question was raised: what about DANE?

Which is a good question. So, I think Google is prepared to
contemplate running a CT log for DANE, but this leaves some
questions...

a) What would we log? DNSSEC keys as well as certs? Only DNSSEC keys?
Something else?

b) How do we prevent the log getting spammed out of existence as soon
as it becomes useful?

c) When someone observes badness in the log, what do they do about it?

I do not intend to drive the answers to these questions, but if
someone supplies them I will certainly consider running a DANE log.

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Subject: Re: [therightkey] [dane] DANE and CT
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On 14 November 2012 16:02, Tony Finch <dot@dotat.at> wrote:
> Ben Laurie <benl@google.com> wrote:
>
>> At the CT BoF the question was raised: what about DANE?
>>
>> Which is a good question. So, I think Google is prepared to
>> contemplate running a CT log for DANE, but this leaves some
>> questions...
>
> What problem would CT for DANE be aiming to fix?

By all means add that to the list of questions :-)

But I assume the same problem CT already fixes: misissuance of certs
(which in the DNSSEC world I guess mostly boils down to bad
delegation).

>
> Tony.
> --
> f.anthony.n.finch  <dot@dotat.at>  http://dotat.at/
> Forties, Cromarty: East, veering southeast, 4 or 5, occasionally 6 at first.
> Rough, becoming slight or moderate. Showers, rain at first. Moderate or good,
> occasionally poor at first.

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Subject: Re: [therightkey] [dane] DANE and CT
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Ben Laurie <benl@google.com> wrote:

> At the CT BoF the question was raised: what about DANE?
>
> Which is a good question. So, I think Google is prepared to
> contemplate running a CT log for DANE, but this leaves some
> questions...

What problem would CT for DANE be aiming to fix?

Tony.
-- 
f.anthony.n.finch  <dot@dotat.at>  http://dotat.at/
Forties, Cromarty: East, veering southeast, 4 or 5, occasionally 6 at first.
Rough, becoming slight or moderate. Showers, rain at first. Moderate or good,
occasionally poor at first.

From warren@kumari.net  Wed Nov 14 08:28:39 2012
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Subject: Re: [therightkey] [dane] DANE and CT
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On Nov 14, 2012, at 11:02 AM, Tony Finch <dot@dotat.at> wrote:

> Ben Laurie <benl@google.com> wrote:
>=20
>> At the CT BoF the question was raised: what about DANE?
>>=20
>> Which is a good question. So, I think Google is prepared to
>> contemplate running a CT log for DANE, but this leaves some
>> questions...
>=20
> What problem would CT for DANE be aiming to fix?
>=20

If I run example.com and someone managed to generate / publish a TLSA =
record for that I'd sure like to know about it.=20
Yes, I should be able to simply check myself (and presumably a malicious =
actor wouldn't submit it to the log :-)), but it seem like it couldn't =
hurt[0]

Also, as a relying party, if I'm checking / relying on CT this gives me =
additional information - if the cert / TLSSA record do not match the =
published stuff in the log I may have evidence that shenanigans are =
afoot.

Yes, there is a fair bit of detail still to be worked out (what do you =
*do* if they don't match? what if a DANE user simply doesn't want to =
publish and the world moves to enforced CT?), the "it seems like it =
can't hurt" feels scary, and so needs more thought, but to me CT and =
DANE seem complementary, not competing technologies=85


W
[0]: Famous last words!

> Tony.
> --=20
> f.anthony.n.finch  <dot@dotat.at>  http://dotat.at/
> Forties, Cromarty: East, veering southeast, 4 or 5, occasionally 6 at =
first.
> Rough, becoming slight or moderate. Showers, rain at first. Moderate =
or good,
> occasionally poor at first.
> _______________________________________________
> dane mailing list
> dane@ietf.org
> https://www.ietf.org/mailman/listinfo/dane
>=20

--
Do not meddle in the affairs of dragons, for you are crunchy and taste =
good with ketchup.=20




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On Wed, 14 Nov 2012, Ben Laurie wrote:

>>> At the CT BoF the question was raised: what about DANE?
>>>
>>> Which is a good question. So, I think Google is prepared to
>>> contemplate running a CT log for DANE, but this leaves some
>>> questions...
>>
>> What problem would CT for DANE be aiming to fix?
>
> By all means add that to the list of questions :-)
>
> But I assume the same problem CT already fixes: misissuance of certs
> (which in the DNSSEC world I guess mostly boils down to bad
> delegation).

Does that make sense though? With RRSIG validity times and TTL's you
can set your "damange period" as small as you want. There is no issue
like with certificates where your credentials can be abused for up to
12 months.

The only use I could see is as an alternative mechanism to transfer these
records into the application that does not require a clean DNS transport.

I think CT is a bandaid for PKIX that does not apply to DANE.

I think the problem with DANE/DNSSEC right now is the additional latency
and dns transport issues (hotspots, VPN, etc) but I don't think CT is
very well suited to address those.

Paul

From benl@google.com  Wed Nov 14 08:35:32 2012
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Date: Wed, 14 Nov 2012 16:35:31 +0000
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Cc: Tony Finch <dot@dotat.at>, therightkey@ietf.org, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane] DANE and CT
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On 14 November 2012 16:30, Paul Wouters <paul@nohats.ca> wrote:
> On Wed, 14 Nov 2012, Ben Laurie wrote:
>
>>>> At the CT BoF the question was raised: what about DANE?
>>>>
>>>> Which is a good question. So, I think Google is prepared to
>>>> contemplate running a CT log for DANE, but this leaves some
>>>> questions...
>>>
>>>
>>> What problem would CT for DANE be aiming to fix?
>>
>>
>> By all means add that to the list of questions :-)
>>
>> But I assume the same problem CT already fixes: misissuance of certs
>> (which in the DNSSEC world I guess mostly boils down to bad
>> delegation).
>
>
> Does that make sense though? With RRSIG validity times and TTL's you
> can set your "damange period" as small as you want. There is no issue
> like with certificates where your credentials can be abused for up to
> 12 months.
>
> The only use I could see is as an alternative mechanism to transfer these
> records into the application that does not require a clean DNS transport.
>
> I think CT is a bandaid for PKIX that does not apply to DANE.
>
> I think the problem with DANE/DNSSEC right now is the additional latency
> and dns transport issues (hotspots, VPN, etc) but I don't think CT is
> very well suited to address those.

a) Why would an attacker use your validity times?

b) Weren't you amongst those asking for CT to support DANE during the BoF?

I disagree that CT is a bandaid for anything, BTW - it is a useful
mechanism in its own right.

From tom@ritter.vg  Wed Nov 14 08:37:39 2012
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From: Tom Ritter <tom@ritter.vg>
Date: Wed, 14 Nov 2012 11:37:17 -0500
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Subject: Re: [therightkey] [dane]  DANE and CT
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On 14 November 2012 11:30, Paul Wouters <paul@nohats.ca> wrote:

> I think CT is a bandaid for PKIX that does not apply to DANE.
>

Perhaps not DANE - but DNSSEC.  PKIX allows N CAs to issue unlimited
trusted certs for your domain.  DNSSEC allows 1 TLD to issue unlimited
trusted signing keys for your domain.  Maybe it's the KSK that should go
into a log?

-tom

--047d7bdc7a9a04ced304ce772724
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On 14 November 2012 11:30, Paul Wouters <span dir=3D"ltr">&lt;<a href=3D"ma=
ilto:paul@nohats.ca" target=3D"_blank">paul@nohats.ca</a>&gt;</span> wrote:=
<br><div class=3D"gmail_extra"><div class=3D"gmail_quote"><blockquote class=
=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1px #ccc solid;padd=
ing-left:1ex">

<div class=3D"im">I think CT is a bandaid for PKIX that does not apply to D=
ANE.</div></blockquote><div><br></div><div>Perhaps not DANE - but DNSSEC. =
=A0PKIX allows N CAs to issue unlimited trusted certs for your domain. =A0D=
NSSEC allows 1 TLD to issue unlimited trusted signing keys for your domain.=
 =A0Maybe it&#39;s the KSK that should go into a log?</div>

<div><br></div><div>-tom</div></div></div>

--047d7bdc7a9a04ced304ce772724--

From fanf2@hermes.cam.ac.uk  Wed Nov 14 09:02:47 2012
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Date: Wed, 14 Nov 2012 17:02:43 +0000
From: Tony Finch <dot@dotat.at>
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Warren Kumari <warren@kumari.net> wrote:
>
> If I run example.com and someone managed to generate / publish a TLSA
> record for that I'd sure like to know about it.

Right. But in PKIX a mis-issued certificate has nothing to do with your
own infrastructure, whereas with DANE it implies that your infrastructure
(or the infrastructure of your DNS service providers) has been
compromised.

I'm a bit worried about the operational implications: PKIX CT is extra
work for CAs, but DANE CT is extra work for everyone.

So I'm skeptical that the cost/benefit tradeoff is positive.

Tony.
-- 
f.anthony.n.finch  <dot@dotat.at>  http://dotat.at/
Forties, Cromarty: East, veering southeast, 4 or 5, occasionally 6 at first.
Rough, becoming slight or moderate. Showers, rain at first. Moderate or good,
occasionally poor at first.

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Date: Wed, 14 Nov 2012 17:07:58 +0000
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Cc: therightkey@ietf.org, Warren Kumari <warren@kumari.net>, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane] DANE and CT
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On 14 November 2012 17:02, Tony Finch <dot@dotat.at> wrote:
> Warren Kumari <warren@kumari.net> wrote:
>>
>> If I run example.com and someone managed to generate / publish a TLSA
>> record for that I'd sure like to know about it.
>
> Right. But in PKIX a mis-issued certificate has nothing to do with your
> own infrastructure, whereas with DANE it implies that your infrastructure
> (or the infrastructure of your DNS service providers) has been
> compromised.

Isn't the infrastructure of your DNS service providers nothing to do
with your own infrastructure? Not to mention your TLD's
infrastructure, and that of all of their registrars (and, presumably,
DNS service providers)?

> I'm a bit worried about the operational implications: PKIX CT is extra
> work for CAs, but DANE CT is extra work for everyone.

Only everyone who uses keys, and they've already signed up for quite a
lot of work.

> So I'm skeptical that the cost/benefit tradeoff is positive.

I am unconvinced by your argument.

>
> Tony.
> --
> f.anthony.n.finch  <dot@dotat.at>  http://dotat.at/
> Forties, Cromarty: East, veering southeast, 4 or 5, occasionally 6 at first.
> Rough, becoming slight or moderate. Showers, rain at first. Moderate or good,
> occasionally poor at first.

From shuque@upenn.edu  Wed Nov 14 09:29:52 2012
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Date: Wed, 14 Nov 2012 12:29:50 -0500
From: Shumon Huque <shuque@upenn.edu>
To: Ben Laurie <benl@google.com>
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References: <CABrd9SRyv+UerPJBf+gw47nWj3t4ekHRnWsKC0pHcadHV5mvmw@mail.gmail.com> <alpine.LSU.2.00.1211141601220.27013@hermes-1.csi.cam.ac.uk> <212E2C13-CE98-43BB-B665-14DD18236F03@kumari.net> <alpine.LSU.2.00.1211141640120.15409@hermes-1.csi.cam.ac.uk> <CABrd9ST8duM=U-0g02yres_qEY5tnLY6dXLJzxcXiKYEqmiFNA@mail.gmail.com>
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Cc: Tony Finch <dot@dotat.at>, therightkey@ietf.org, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane] DANE and CT
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On Wed, Nov 14, 2012 at 05:07:58PM +0000, Ben Laurie wrote:
> On 14 November 2012 17:02, Tony Finch <dot@dotat.at> wrote:
> > Warren Kumari <warren@kumari.net> wrote:
> >>
> >> If I run example.com and someone managed to generate / publish a TLSA
> >> record for that I'd sure like to know about it.
> >
> > Right. But in PKIX a mis-issued certificate has nothing to do with your
> > own infrastructure, whereas with DANE it implies that your infrastructure
> > (or the infrastructure of your DNS service providers) has been
> > compromised.
> 
> Isn't the infrastructure of your DNS service providers nothing to do
> with your own infrastructure? Not to mention your TLD's
> infrastructure, and that of all of their registrars (and, presumably,
> DNS service providers)?

One critical difference is that with DANE, I can query the DNSSEC
delegation chain myself and detect whether my TLD has installed a
bogus DS record and take action. I cannot today detect a bogus 
X.509 cert by myself. I think this makes a CT like scheme less necessary 
for DANE.

-- 
Shumon Huque
University of Pennsylvania.

From tom@ritter.vg  Wed Nov 14 09:51:29 2012
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Subject: Re: [therightkey] [dane] DANE and CT
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--14dae9cdca9be5de6304ce782edd
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On 14 November 2012 12:29, Shumon Huque <shuque@upenn.edu> wrote:

> One critical difference is that with DANE, I can query the DNSSEC
> delegation chain myself and detect whether my TLD has installed a
> bogus DS record and take action. I cannot today detect a bogus
> X.509 cert by myself. I think this makes a CT like scheme less necessary
> for DANE.


I can query my server on port 443 and see if there is a bogus certificate.
 The lack of a bogus certificate in a response to a single query does not
mean there is not a valid attacker-controlled signature chain an attacker
could send to attack a user - whether that signature chain is of PKIX
signatures or DNSSEC signatures.

-tom

--14dae9cdca9be5de6304ce782edd
Content-Type: text/html; charset=ISO-8859-1
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On 14 November 2012 12:29, Shumon Huque <span dir=3D"ltr">&lt;<a href=3D"ma=
ilto:shuque@upenn.edu" target=3D"_blank">shuque@upenn.edu</a>&gt;</span> wr=
ote:<br><div class=3D"gmail_extra"><div class=3D"gmail_quote"><blockquote c=
lass=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1px #ccc solid;=
padding-left:1ex">

<div class=3D"im">One critical difference is that with DANE, I can query th=
e DNSSEC<br></div>
delegation chain myself and detect whether my TLD has installed a<br>
bogus DS record and take action. I cannot today detect a bogus<br>
X.509 cert by myself. I think this makes a CT like scheme less necessary<br=
>
for DANE.</blockquote><div><br></div><div>I can query my server on port 443=
 and see if there is a bogus certificate. =A0The lack of a bogus certificat=
e in a response to a single query does not mean there is not a valid attack=
er-controlled signature chain an attacker could send to attack a user - whe=
ther that signature chain is of PKIX signatures or DNSSEC signatures.</div>

<div><br></div><div>-tom</div></div></div>

--14dae9cdca9be5de6304ce782edd--

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Subject: Re: [therightkey] [dane] DANE and CT
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On 14 November 2012 17:29, Shumon Huque <shuque@upenn.edu> wrote:
> On Wed, Nov 14, 2012 at 05:07:58PM +0000, Ben Laurie wrote:
>> On 14 November 2012 17:02, Tony Finch <dot@dotat.at> wrote:
>> > Warren Kumari <warren@kumari.net> wrote:
>> >>
>> >> If I run example.com and someone managed to generate / publish a TLSA
>> >> record for that I'd sure like to know about it.
>> >
>> > Right. But in PKIX a mis-issued certificate has nothing to do with your
>> > own infrastructure, whereas with DANE it implies that your infrastructure
>> > (or the infrastructure of your DNS service providers) has been
>> > compromised.
>>
>> Isn't the infrastructure of your DNS service providers nothing to do
>> with your own infrastructure? Not to mention your TLD's
>> infrastructure, and that of all of their registrars (and, presumably,
>> DNS service providers)?
>
> One critical difference is that with DANE, I can query the DNSSEC
> delegation chain myself and detect whether my TLD has installed a
> bogus DS record and take action. I cannot today detect a bogus
> X.509 cert by myself. I think this makes a CT like scheme less necessary
> for DANE.

You can't detect a bogus X.509 cert because you can't connect to the
server serving it, presumably. What magic allows you to perform this
trick for DNS but not HTTPS?

>
> --
> Shumon Huque
> University of Pennsylvania.

From carl@redhoundsoftware.com  Wed Nov 14 09:57:19 2012
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From: Carl Wallace <carl@redhoundsoftware.com>
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Subject: Re: [therightkey] [dane]   DANE and CT
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On 11/14/12 11:30 AM, "Paul Wouters" <paul@nohats.ca> wrote:

<snip>
>I think CT is a bandaid for PKIX that does not apply to DANE.

I thought the point was that DANE would not be allowed to do "an end run"
around CT so logging DANE stuff was necessary, not that DANE necessarily
had the same needs as the web PKI.



From shuque@upenn.edu  Wed Nov 14 10:14:39 2012
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From: Shumon Huque <shuque@upenn.edu>
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References: <CABrd9SRyv+UerPJBf+gw47nWj3t4ekHRnWsKC0pHcadHV5mvmw@mail.gmail.com> <alpine.LSU.2.00.1211141601220.27013@hermes-1.csi.cam.ac.uk> <212E2C13-CE98-43BB-B665-14DD18236F03@kumari.net> <alpine.LSU.2.00.1211141640120.15409@hermes-1.csi.cam.ac.uk> <CABrd9ST8duM=U-0g02yres_qEY5tnLY6dXLJzxcXiKYEqmiFNA@mail.gmail.com> <20121114172950.GA13499@isc.upenn.edu> <CABrd9SSMq8RQVTB7OWHEULC0Kwy-XqXEiKzEE5e6O7cG1_6Hiw@mail.gmail.com>
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Cc: Tony Finch <dot@dotat.at>, therightkey@ietf.org, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane] DANE and CT
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On Wed, Nov 14, 2012 at 05:56:24PM +0000, Ben Laurie wrote:
> On 14 November 2012 17:29, Shumon Huque <shuque@upenn.edu> wrote:
> > On Wed, Nov 14, 2012 at 05:07:58PM +0000, Ben Laurie wrote:
> >> On 14 November 2012 17:02, Tony Finch <dot@dotat.at> wrote:
> >> > Warren Kumari <warren@kumari.net> wrote:
> >> >>
> >> >> If I run example.com and someone managed to generate / publish a TLSA
> >> >> record for that I'd sure like to know about it.
> >> >
> >> > Right. But in PKIX a mis-issued certificate has nothing to do with your
> >> > own infrastructure, whereas with DANE it implies that your infrastructure
> >> > (or the infrastructure of your DNS service providers) has been
> >> > compromised.
> >>
> >> Isn't the infrastructure of your DNS service providers nothing to do
> >> with your own infrastructure? Not to mention your TLD's
> >> infrastructure, and that of all of their registrars (and, presumably,
> >> DNS service providers)?
> >
> > One critical difference is that with DANE, I can query the DNSSEC
> > delegation chain myself and detect whether my TLD has installed a
> > bogus DS record and take action. I cannot today detect a bogus
> > X.509 cert by myself. I think this makes a CT like scheme less necessary
> > for DANE.
> 
> You can't detect a bogus X.509 cert because you can't connect to the
> server serving it, presumably. What magic allows you to perform this
> trick for DNS but not HTTPS?

For the DANE/DNSSEC case, I'm detecting an attack on the DNSSEC 
authentication chain, not the existence of a fraudulently issued 
certificate on some attacker's server.

If the DNSSEC chain is intact, then presumably DANE aware clients 
will properly authenticate the TLSA record before accepting the server 
certificate. I admit that's a mighty presumption today, but we'll see ...

-- 
Shumon Huque
University of Pennsylvania.

From fneves@registro.br  Wed Nov 14 10:49:03 2012
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Subject: Re: [therightkey] [dane]   DANE and CT
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On Wed, Nov 14, 2012 at 04:35:31PM +0000, Ben Laurie wrote:
> On 14 November 2012 16:30, Paul Wouters <paul@nohats.ca> wrote:
> > On Wed, 14 Nov 2012, Ben Laurie wrote:
...
> >>> What problem would CT for DANE be aiming to fix?
> >>
> >>
> >> By all means add that to the list of questions :-)
> >>
> >> But I assume the same problem CT already fixes: misissuance of certs
> >> (which in the DNSSEC world I guess mostly boils down to bad
> >> delegation).
> >
> >
> > Does that make sense though? With RRSIG validity times and TTL's you
> > can set your "damange period" as small as you want. There is no issue
> > like with certificates where your credentials can be abused for up to
> > 12 months.
> >
> > The only use I could see is as an alternative mechanism to transfer these
> > records into the application that does not require a clean DNS transport.
> >
> > I think CT is a bandaid for PKIX that does not apply to DANE.
> >
> > I think the problem with DANE/DNSSEC right now is the additional latency
> > and dns transport issues (hotspots, VPN, etc) but I don't think CT is
> > very well suited to address those.
> 
> a) Why would an attacker use your validity times?

What do you mean? What is your attack scenario? This thread quickly
starts to move to a marshy soil.

Fred

From chris@randomnonce.org  Wed Nov 14 18:09:56 2012
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Subject: [therightkey] draft-laurie-pki-sunlight-02
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I have a few questions and comments on this document:

A general comment: What should a log do if it receives multiple
submissions of the same certificate?  It MUST detect and reject
duplicates?  SHOULD detect?  What if it receives a certificate
containing an embedded SCT from itself?  MUST/SHOULD/MAY reject?

Section 1.1 fixes the hash algorithm as SHA-256.  It makes no mention
of acceptable digital signature algorithms.
http://www.certificate-transparency.org/sizes indicates the thinking
is ECC.  Is RSA an acceptable signature algorithm?

Section 2.1: Shouldn't Version be covered by the signature in a
SignedCertificateTimestamp?  I'd think it would be beneficial to be
able to verify that the signature was intended for the same version as
is claimed in the unsigned portion.

Section 2.2 (minor edit): upon first read, the units of old_tree_size
wasn't clear (leaf count?  bytes?)  The description of tree_size is
explicit on the units ("number of entries").  I would appreciate it if
old_tree_size had similar text.

Section 2.3 (minor edit): the last bullet uses the term
tree_signature, when the rest of the text uses tree_head_signature.

Regards,
Chris

From hallam@gmail.com  Thu Nov 15 05:02:07 2012
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On Wed, Nov 14, 2012 at 11:02 AM, Tony Finch <dot@dotat.at> wrote:

> Ben Laurie <benl@google.com> wrote:
>
> > At the CT BoF the question was raised: what about DANE?
> >
> > Which is a good question. So, I think Google is prepared to
> > contemplate running a CT log for DANE, but this leaves some
> > questions...
>
> What problem would CT for DANE be aiming to fix?
>

I see a number of issues that need fixing:

1) Domain hijacking

DANE certificates are only as secure as the DNS names they are attached to.
DNS hijacking occurs at a rate well in excess of 10,000 names a year and is
probably much much higher if we could get better numbers.

At present the DNS name owner (and it is the owner, regardless of what
idiot lawyers claim) has to rely on their registrar to be competent and on
the processes at the registry and to a certain extent on the honesty of
other registrars. This whole area is essentially opaque, there is no
documentation for most of the processes on which businesses are forced to
rely.


2) Root jacking

Russia and China are just not going to be recognizing the ICANN roots
dudes. They have been telling everyone who will listen that they are going
to fork the root and they have a big enough fraction of the population of
the planet to make it stick.

So people can do the ostrich head in the sand thing or they can anticipate
this attack and think about ways to neutralize it.


3) Demonstrate continuity

In the case that a DNS name changes hands I do not necessarily want to be
sending the new information the confidential data I would have sent the old
one. Lacking the ability to establish an external validation of the source,
this means I am much more interested in determining the lineage of
credentials.


Or it could just be that the DANE people have created an absolutely perfect
system that is beyond any possible reproach and the fact that nobody seems
to be implementing it beyond limited scale trials and plugins is due to the
inability of everyone else to fully appreciate their awesomeness.


-- 
Website: http://hallambaker.com/

--e89a8fb2007c068a1004ce884299
Content-Type: text/html; charset=ISO-8859-1
Content-Transfer-Encoding: quoted-printable

<br><br><div class=3D"gmail_quote">On Wed, Nov 14, 2012 at 11:02 AM, Tony F=
inch <span dir=3D"ltr">&lt;<a href=3D"mailto:dot@dotat.at" target=3D"_blank=
">dot@dotat.at</a>&gt;</span> wrote:<br><blockquote class=3D"gmail_quote" s=
tyle=3D"margin:0 0 0 .8ex;border-left:1px #ccc solid;padding-left:1ex">
<div class=3D"im">Ben Laurie &lt;<a href=3D"mailto:benl@google.com">benl@go=
ogle.com</a>&gt; wrote:<br>
<br>
&gt; At the CT BoF the question was raised: what about DANE?<br>
&gt;<br>
&gt; Which is a good question. So, I think Google is prepared to<br>
&gt; contemplate running a CT log for DANE, but this leaves some<br>
&gt; questions...<br>
<br>
</div>What problem would CT for DANE be aiming to fix?<br></blockquote><div=
><br></div><div>I see a number of issues that need fixing:</div><div><br></=
div><div>1) Domain hijacking</div><div><br></div><div>DANE certificates are=
 only as secure as the DNS names they are attached to. DNS hijacking occurs=
 at a rate well in excess of 10,000 names a year and is probably much much =
higher if we could get better numbers.</div>
<div><br></div><div>At present the DNS name owner (and it is the owner, reg=
ardless of what idiot lawyers claim) has to rely on their registrar to be c=
ompetent and on the processes at the registry and to a certain extent on th=
e honesty of other registrars. This whole area is essentially opaque, there=
 is no documentation for most of the processes on which businesses are forc=
ed to rely.</div>
<div><br></div><div><br></div><div>2) Root jacking</div><div><br></div><div=
>Russia and China are just not going to be recognizing the ICANN roots dude=
s. They have been telling everyone who will listen that they are going to f=
ork the root and they have a big enough fraction of the population of the p=
lanet to make it stick.</div>
<div><br></div><div>So people can do the ostrich head in the sand thing or =
they can anticipate this attack and think about ways to neutralize it.</div=
><div><br></div><div><br></div><div>3) Demonstrate continuity</div><div>
<br></div><div>In the case that a DNS name changes hands I do not necessari=
ly want to be sending the new information the confidential data I would hav=
e sent the old one. Lacking the ability to establish an external validation=
 of the source, this means I am much more interested in determining the lin=
eage of credentials.</div>
<div><br></div><div><br></div><div>Or it could just be that the DANE people=
 have created an absolutely perfect system that is beyond any possible repr=
oach and the fact that nobody seems to be implementing it beyond limited sc=
ale trials and plugins is due to the inability of everyone else to fully ap=
preciate their awesomeness.</div>
<div>=A0</div></div><div><br></div>-- <br>Website: <a href=3D"http://hallam=
baker.com/">http://hallambaker.com/</a><br><br>

--e89a8fb2007c068a1004ce884299--

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Subject: Re: [therightkey] draft-laurie-pki-sunlight-02
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On 15 November 2012 02:09, Chris Richardson <chris@randomnonce.org> wrote:
> I have a few questions and comments on this document:
>
> A general comment: What should a log do if it receives multiple
> submissions of the same certificate?  It MUST detect and reject
> duplicates?  SHOULD detect?  What if it receives a certificate
> containing an embedded SCT from itself?  MUST/SHOULD/MAY reject?

MAY return the same SCT as last time - this is already fixed in the
next version (which I couldn't submit coz of cutoff dates).

> Section 1.1 fixes the hash algorithm as SHA-256.  It makes no mention
> of acceptable digital signature algorithms.
> http://www.certificate-transparency.org/sizes indicates the thinking
> is ECC.  Is RSA an acceptable signature algorithm?

Yes, but obviously expensive, since a certificate should usually
contain more than one SCT.

>
> Section 2.1: Shouldn't Version be covered by the signature in a
> SignedCertificateTimestamp?  I'd think it would be beneficial to be
> able to verify that the signature was intended for the same version as
> is claimed in the unsigned portion.

Yes, this is already fixed, also.

> Section 2.2 (minor edit): upon first read, the units of old_tree_size
> wasn't clear (leaf count?  bytes?)  The description of tree_size is
> explicit on the units ("number of entries").  I would appreciate it if
> old_tree_size had similar text.

OK.

> Section 2.3 (minor edit): the last bullet uses the term
> tree_signature, when the rest of the text uses tree_head_signature.

Oops.

I'm travelling this week, but will try to get an update out next week.

>
> Regards,
> Chris
> _______________________________________________
> therightkey mailing list
> therightkey@ietf.org
> https://www.ietf.org/mailman/listinfo/therightkey

From paul.hoffman@vpnc.org  Thu Nov 15 07:46:44 2012
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References: <CABrd9SRyv+UerPJBf+gw47nWj3t4ekHRnWsKC0pHcadHV5mvmw@mail.gmail.com> <alpine.LSU.2.00.1211141601220.27013@hermes-1.csi.cam.ac.uk> <212E2C13-CE98-43BB-B665-14DD18236F03@kumari.net> <alpine.LSU.2.00.1211141640120.15409@hermes-1.csi.cam.ac.uk> <CABrd9ST8duM=U-0g02yres_qEY5tnLY6dXLJzxcXiKYEqmiFNA@mail.gmail.com> <20121114172950.GA13499@isc.upenn.edu> <CABrd9SSMq8RQVTB7OWHEULC0Kwy-XqXEiKzEE5e6O7cG1_6Hiw@mail.gmail.com> <20121114181437.GA26508@isc.upenn.edu>
To: Shumon Huque <shuque@upenn.edu>
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Cc: therightkey@ietf.org, Ben Laurie <benl@google.com>, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane]   DANE and CT
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On Nov 14, 2012, at 10:14 AM, Shumon Huque <shuque@upenn.edu> wrote:

> For the DANE/DNSSEC case, I'm detecting an attack on the DNSSEC=20
> authentication chain, not the existence of a fraudulently issued=20
> certificate on some attacker's server.
>=20
> If the DNSSEC chain is intact, then presumably DANE aware clients=20
> will properly authenticate the TLSA record before accepting the server=20=

> certificate. I admit that's a mighty presumption today, but we'll see =
...

This is an excellent summary of the scenario.

However, that's not exactly what Ben is asking about. CT-for-PKIX is =
about "did a trusted CA issue a certificate it should not have". =
CT-for-DNSSEC is about "did a server in the hierarchy above the leaf =
include a DS it should not have". In the latter case, those rogue DS =
records might not be detectable to the party with the leaf record.

For example, assume the domain name example.newtld. The owner of example =
has put DS record A in the newtld zone. If the owner of newtld goes =
rogue and shows DS record B to a limited number of requests (such as to =
a particular geographic region or set of network addresses), the party =
with the private key associated with B can spoof example, and the owner =
of example would not know unless he could see B.

--Paul Hoffman=

From shuque@upenn.edu  Thu Nov 15 10:43:25 2012
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From: Shumon Huque <shuque@upenn.edu>
To: Paul Hoffman <paul.hoffman@vpnc.org>
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References: <CABrd9SRyv+UerPJBf+gw47nWj3t4ekHRnWsKC0pHcadHV5mvmw@mail.gmail.com> <alpine.LSU.2.00.1211141601220.27013@hermes-1.csi.cam.ac.uk> <212E2C13-CE98-43BB-B665-14DD18236F03@kumari.net> <alpine.LSU.2.00.1211141640120.15409@hermes-1.csi.cam.ac.uk> <CABrd9ST8duM=U-0g02yres_qEY5tnLY6dXLJzxcXiKYEqmiFNA@mail.gmail.com> <20121114172950.GA13499@isc.upenn.edu> <CABrd9SSMq8RQVTB7OWHEULC0Kwy-XqXEiKzEE5e6O7cG1_6Hiw@mail.gmail.com> <20121114181437.GA26508@isc.upenn.edu> <CF602349-8B21-4429-B518-AFD17D6E72FC@vpnc.org>
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Cc: therightkey@ietf.org, Ben Laurie <benl@google.com>, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane]   DANE and CT
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On Thu, Nov 15, 2012 at 07:46:47AM -0800, Paul Hoffman wrote:
> On Nov 14, 2012, at 10:14 AM, Shumon Huque <shuque@upenn.edu> wrote:
> 
> > For the DANE/DNSSEC case, I'm detecting an attack on the DNSSEC 
> > authentication chain, not the existence of a fraudulently issued 
> > certificate on some attacker's server.
> > 
> > If the DNSSEC chain is intact, then presumably DANE aware clients 
> > will properly authenticate the TLSA record before accepting the server 
> > certificate. I admit that's a mighty presumption today, but we'll see ...
> 
> This is an excellent summary of the scenario.
> 
> However, that's not exactly what Ben is asking about. CT-for-PKIX is about "did a trusted CA issue a certificate it should not have". CT-for-DNSSEC is about "did a server in the hierarchy above the leaf include a DS it should not have". In the latter case, those rogue DS records might not be detectable to the party with the leaf record.
> 
> For example, assume the domain name example.newtld. The owner of example has put DS record A in the newtld zone. If the owner of newtld goes rogue and shows DS record B to a limited number of requests (such as to a particular geographic region or set of network addresses), the party with the private key associated with B can spoof example, and the owner of example would not know unless he could see B.
> 
> --Paul Hoffman

Good point. An auditable log of DS/SEP key chains would seem to
be useful for this.

-- 
Shumon Huque
University of Pennsylvania.

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Cc: Tony Finch <dot@dotat.at>, therightkey@ietf.org, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane] DANE and CT
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On Wed, 14 Nov 2012, Ben Laurie wrote:

>> I think CT is a bandaid for PKIX that does not apply to DANE.
>>
>> I think the problem with DANE/DNSSEC right now is the additional latency
>> and dns transport issues (hotspots, VPN, etc) but I don't think CT is
>> very well suited to address those.
>
> a) Why would an attacker use your validity times?

Because there are DNSSEC keys to back the time slots used, and
without it, the data can and should be rejected.

> b) Weren't you amongst those asking for CT to support DANE during the BoF?

I wanted CT to not exclude DANE, and thereby enforcing an artificial TLS
certificate market where I have to pay $10-$150 a year to be "accepted"
in browsers via CT. What I understood was that browser vendors that
were looking at CT and DANE would specifically not be supoprted. The
first thought was to have a DANE backed CT that could be configured,
purely to get the DANE information (valid key + TTL/RRSIG info) into
the browsers that don't support or want to support DNSSEC (chains).

But the DANE/DNSSEC information does not need an publicly shared audit
log. Its current up to date  validity is available in the DNS at all
times, cached and distributed.

Paul

From paul@nohats.ca  Thu Nov 15 12:33:34 2012
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Cc: therightkey@ietf.org, Shumon Huque <shuque@upenn.edu>, Ben Laurie <benl@google.com>, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane]   DANE and CT
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On Thu, 15 Nov 2012, Paul Hoffman wrote:

> On Nov 14, 2012, at 10:14 AM, Shumon Huque <shuque@upenn.edu> wrote:
>
>> For the DANE/DNSSEC case, I'm detecting an attack on the DNSSEC
>> authentication chain, not the existence of a fraudulently issued
>> certificate on some attacker's server.
>>
>> If the DNSSEC chain is intact, then presumably DANE aware clients
>> will properly authenticate the TLSA record before accepting the server
>> certificate. I admit that's a mighty presumption today, but we'll see ...
>
> This is an excellent summary of the scenario.
>
> However, that's not exactly what Ben is asking about. CT-for-PKIX is about "did a trusted CA issue a certificate it should not have". CT-for-DNSSEC is about "did a server in the hierarchy above the leaf include a DS it should not have". In the latter case, those rogue DS records might not be detectable to the party with the leaf record.
>
> For example, assume the domain name example.newtld. The owner of example has put DS record A in the newtld zone. If the owner of newtld goes rogue and shows DS record B to a limited number of requests (such as to a particular geographic region or set of network addresses), the party with the private key associated with B can spoof example, and the owner of example would not know unless he could see B.

Interesting. I had not considered this because a big difference is that
such rogue DNS records would not be contained/targetted. The forged DS
created by the parent would quickly expose the parent, and I doubt the
parents would want that reputation damage. Unless they are totalitarian
governments, but unlike phb, I give up any kind of using the internet
against advisaries that are physically in the path - it just ends up
with you refusing to be lied to and not connecting, or going along with
their lies and getting eavesdropped.

But I'm not sure how CT would see the difference between me logging
in to my registrar interface and updating the DS record, someone else
using my credentials to do the same without my knowledge, or the registry
going rogue. The way PKIX-CT does this is via some financial transaction
pretending to convey trust and authority and a credit card audit trail.
It fails for the common user precisely because it costs money, and
today's criminals have more money to invest compared to the average
internet user.

I also don't see how TACK addresses this either, with their complicated
pinning schemes that are just many different ways of shooting yourself
in the foot, without adding anything to the DANE pinning method (apart
from relying on verisign to not forfeit their root zone contract to sign
custom data for anyone)

So I think CT could be used as DNSSEC/DANE history audit log, but IMHO
the main asset of something like CT based DANE is purely as a better transport
layer for DNSSEC - not as a replacement for DANE/DNSSEC.

DNSSEC points to the publisher, who is defined as always right (even if
they are wrong because they are sloppy or have a gun pointed at their
heads)

Paul


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Subject: Re: [therightkey] [dane] DANE and CT
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On Nov 15, 2012, at 8:02 AM, Phillip Hallam-Baker wrote:

>=20
> DANE certificates are only as secure as the DNS names they are =
attached to. DNS hijacking occurs at a rate well in excess of 10,000 =
names a year and is probably much much higher if we could get better =
numbers.

PHB - do you have a citation qualifying this?

Thanks,=20

-danny



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Subject: Re: [therightkey] [dane] DANE and CT
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--e89a8ff253583af9ed04ce91a61f
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On Thu, Nov 15, 2012 at 5:57 PM, Danny McPherson <danny@tcb.net> wrote:

>
> On Nov 15, 2012, at 8:02 AM, Phillip Hallam-Baker wrote:
>
> >
> > DANE certificates are only as secure as the DNS names they are attached
> to. DNS hijacking occurs at a rate well in excess of 10,000 names a year
> and is probably much much higher if we could get better numbers.
>
> PHB - do you have a citation qualifying this?
>

Not one I can share. But it seemed at the lower bound to me given the
number of sites I use that have been hijacked recently.

You folk should have much more accurate figures. Care to share?



-- 
Website: http://hallambaker.com/

--e89a8ff253583af9ed04ce91a61f
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<br><br><div class=3D"gmail_quote">On Thu, Nov 15, 2012 at 5:57 PM, Danny M=
cPherson <span dir=3D"ltr">&lt;<a href=3D"mailto:danny@tcb.net" target=3D"_=
blank">danny@tcb.net</a>&gt;</span> wrote:<br><blockquote class=3D"gmail_qu=
ote" style=3D"margin:0 0 0 .8ex;border-left:1px #ccc solid;padding-left:1ex=
">
<div class=3D"im"><br>
On Nov 15, 2012, at 8:02 AM, Phillip Hallam-Baker wrote:<br>
<br>
&gt;<br>
&gt; DANE certificates are only as secure as the DNS names they are attache=
d to. DNS hijacking occurs at a rate well in excess of 10,000 names a year =
and is probably much much higher if we could get better numbers.<br>
<br>
</div>PHB - do you have a citation qualifying this?<br></blockquote><div><b=
r></div><div>Not one I can share. But it seemed at the lower bound to me gi=
ven the number of sites I use that have been hijacked recently.</div><div>
<br></div><div>You folk should have much more accurate figures. Care to sha=
re?=A0</div></div><br><br clear=3D"all"><div><br></div>-- <br>Website: <a h=
ref=3D"http://hallambaker.com/">http://hallambaker.com/</a><br><br>

--e89a8ff253583af9ed04ce91a61f--

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Cc: therightkey@ietf.org, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane] DANE and CT
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On Nov 15, 2012, at 7:14 PM, Phillip Hallam-Baker wrote:

>=20
> You folk should have much more accurate figures. Care to share?=20

Nope, we're just the registry operator, most of these issues are =
resolved with the registrars, hence my query.

Thanks,=20

-danny






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Date: Fri, 16 Nov 2012 11:23:09 +0000
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From: Ben Laurie <benl@google.com>
To: Paul Wouters <paul@nohats.ca>
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Cc: Tony Finch <dot@dotat.at>, therightkey@ietf.org, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane] DANE and CT
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On 15 November 2012 20:10, Paul Wouters <paul@nohats.ca> wrote:
> On Wed, 14 Nov 2012, Ben Laurie wrote:
>
>>> I think CT is a bandaid for PKIX that does not apply to DANE.
>>>
>>> I think the problem with DANE/DNSSEC right now is the additional latency
>>> and dns transport issues (hotspots, VPN, etc) but I don't think CT is
>>> very well suited to address those.
>>
>>
>> a) Why would an attacker use your validity times?
>
>
> Because there are DNSSEC keys to back the time slots used, and
> without it, the data can and should be rejected.

This argument is circular: clearly if no-one ever gets control of keys
for your domain, you don't have a problem. Validity times are
irrelevant.

If someone does get control, they control validity times, no?

>> b) Weren't you amongst those asking for CT to support DANE during the BoF?
>
> I wanted CT to not exclude DANE, and thereby enforcing an artificial TLS
> certificate market where I have to pay $10-$150 a year to be "accepted"
> in browsers via CT. What I understood was that browser vendors that
> were looking at CT and DANE would specifically not be supoprted. The
> first thought was to have a DANE backed CT that could be configured,
> purely to get the DANE information (valid key + TTL/RRSIG info) into
> the browsers that don't support or want to support DNSSEC (chains).
>
> But the DANE/DNSSEC information does not need an publicly shared audit
> log. Its current up to date  validity is available in the DNS at all
> times, cached and distributed.

You have a lot of faith in a mechanism that is not designed to provide
a globally consistent view. How does DNS prevent bad actors from
showing local views of the DNS? (Hint: it doesn't).

This is precisely what CT does, and is exactly the value it adds to
this kind of system.

As for CT vs DANE, it is precisely because DNS does not provide a
robust infrastructure that DANE cannot be allowed to override CT. This
can be fixed by making DANE use some kind of equivalently strong
transparency. I agree with others that this is probably better applied
to DS records than to TLSA records.

>
> Paul

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Cc: therightkey@ietf.org, Shumon Huque <shuque@upenn.edu>, Paul Hoffman <paul.hoffman@vpnc.org>, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane] DANE and CT
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On 15 November 2012 20:32, Paul Wouters <paul@nohats.ca> wrote:
> On Thu, 15 Nov 2012, Paul Hoffman wrote:
>
>> On Nov 14, 2012, at 10:14 AM, Shumon Huque <shuque@upenn.edu> wrote:
>>
>>> For the DANE/DNSSEC case, I'm detecting an attack on the DNSSEC
>>> authentication chain, not the existence of a fraudulently issued
>>> certificate on some attacker's server.
>>>
>>> If the DNSSEC chain is intact, then presumably DANE aware clients
>>> will properly authenticate the TLSA record before accepting the server
>>> certificate. I admit that's a mighty presumption today, but we'll see ...
>>
>>
>> This is an excellent summary of the scenario.
>>
>> However, that's not exactly what Ben is asking about. CT-for-PKIX is about
>> "did a trusted CA issue a certificate it should not have". CT-for-DNSSEC is
>> about "did a server in the hierarchy above the leaf include a DS it should
>> not have". In the latter case, those rogue DS records might not be
>> detectable to the party with the leaf record.
>>
>> For example, assume the domain name example.newtld. The owner of example
>> has put DS record A in the newtld zone. If the owner of newtld goes rogue
>> and shows DS record B to a limited number of requests (such as to a
>> particular geographic region or set of network addresses), the party with
>> the private key associated with B can spoof example, and the owner of
>> example would not know unless he could see B.
>
>
> Interesting. I had not considered this because a big difference is that
> such rogue DNS records would not be contained/targetted. The forged DS
> created by the parent would quickly expose the parent, and I doubt the
> parents would want that reputation damage. Unless they are totalitarian
> governments, but unlike phb, I give up any kind of using the internet
> against advisaries that are physically in the path - it just ends up
> with you refusing to be lied to and not connecting, or going along with
> their lies and getting eavesdropped.
>
> But I'm not sure how CT would see the difference between me logging
> in to my registrar interface and updating the DS record, someone else
> using my credentials to do the same without my knowledge, or the registry
> going rogue. The way PKIX-CT does this is via some financial transaction
> pretending to convey trust and authority and a credit card audit trail.
> It fails for the common user precisely because it costs money, and
> today's criminals have more money to invest compared to the average
> internet user.

Incorrect: CT provides a globally verifiable audit trail - the
exchange of money is irrelevant.

CT does not see the difference between you logging in to your
registrar interface and updating the DS record, someone else using
your credentials to do the same without your knowledge, or the
registry going rogue. What it does it make all of these visible to
you. Then it is up to you (or anyone else) to spot the abuse and do
something about it.

> I also don't see how TACK addresses this either, with their complicated
> pinning schemes that are just many different ways of shooting yourself
> in the foot, without adding anything to the DANE pinning method (apart
> from relying on verisign to not forfeit their root zone contract to sign
> custom data for anyone)
>
> So I think CT could be used as DNSSEC/DANE history audit log, but IMHO
> the main asset of something like CT based DANE is purely as a better
> transport
> layer for DNSSEC - not as a replacement for DANE/DNSSEC.

CT does not replace DNSSEC (or PKIX), it does as you say: provides an audit log.

> DNSSEC points to the publisher, who is defined as always right (even if
> they are wrong because they are sloppy or have a gun pointed at their
> heads)
>
> Paul
>

From paul@nohats.ca  Fri Nov 16 10:50:19 2012
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From: Paul Wouters <paul@nohats.ca>
To: Ben Laurie <benl@google.com>
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Cc: Tony Finch <dot@dotat.at>, therightkey@ietf.org, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane] DANE and CT
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On Fri, 16 Nov 2012, Ben Laurie wrote:

>> Because there are DNSSEC keys to back the time slots used, and
>> without it, the data can and should be rejected.
>
> This argument is circular: clearly if no-one ever gets control of keys
> for your domain, you don't have a problem. Validity times are
> irrelevant.
>
> If someone does get control, they control validity times, no?

If someone obtains your private keys, there is no need to forge anything
or issue any new certificates, they just run a copy of your private
key/cert on their MITM box. CT can't help you there either. If attackers
get your private DNSSEC keys (which shouldn't even be online, and surely
much harder to obtain compared to the TLS private key) you are lost.

> You have a lot of faith in a mechanism that is not designed to provide
> a globally consistent view. How does DNS prevent bad actors from
> showing local views of the DNS? (Hint: it doesn't).

The root key protects me against that. And the TLD key. Sure, if I'm
using some untrusted national TLD which might be overwriting my parent
NS/DS set, again you are in a no-win situation. Best you can do is
monitor your own zone, and possible carry your own domain's trust
anchors with you. And these same players would simply prevent you from
accessing the CT services as well.

> This is precisely what CT does, and is exactly the value it adds to
> this kind of system.
>
> As for CT vs DANE, it is precisely because DNS does not provide a
> robust infrastructure that DANE cannot be allowed to override CT.

So Diginotar will submit a new cert for me to the CT, and we're back at
square one?

> This
> can be fixed by making DANE use some kind of equivalently strong
> transparency. I agree with others that this is probably better applied
> to DS records than to TLSA records.

While I agree that it won't hurt to log and audit DS records to see if
verisign or the USG really is signing their own records with the root or
.com keys, I still believe those two parts are the most secure players
I know to delegate some trust to. The real weak points of DNSSEC will be
the dns operators of the zones and the registrar webgui's for making
zone changes. In fact, I would probably rather trust the root key, then
most CT audit people - and it would come with less false positives due
to the middle man delays.

Paul

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From: Paul Wouters <paul@nohats.ca>
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Cc: therightkey@ietf.org, Shumon Huque <shuque@upenn.edu>, Paul Hoffman <paul.hoffman@vpnc.org>, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane] DANE and CT
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> Incorrect: CT provides a globally verifiable audit trail - the
> exchange of money is irrelevant.

It is if Google CT only accepts submissions of CAs, and Chrome ships
with the Google CT. It forces me to use CAs.

> CT does not see the difference between you logging in to your
> registrar interface and updating the DS record, someone else using
> your credentials to do the same without your knowledge, or the
> registry going rogue. What it does it make all of these visible to
> you. Then it is up to you (or anyone else) to spot the abuse and do
> something about it.

Which is the exact problem of outsourcing trust vs trusting no one.
People keep insisting they can do both. Adding another "cert patrol"
warning box in my browser isn't going to make users more secure. So what
happens if I update my TLS key? I need to live with a few hours of users
getting told my site is hacked and clicking OK, or do we ignore the
first few hours of a site being compromised?

Paul

From paul.hoffman@vpnc.org  Fri Nov 16 11:06:53 2012
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Subject: Re: [therightkey] [dane]   DANE and CT
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On Nov 16, 2012, at 3:23 AM, Ben Laurie <benl@google.com> wrote:

> As for CT vs DANE, it is precisely because DNS does not provide a
> robust infrastructure that DANE cannot be allowed to override CT. This
> can be fixed by making DANE use some kind of equivalently strong
> transparency. I agree with others that this is probably better applied
> to DS records than to TLSA records.

Proposal: we take this off the DANE list and keep it on therightkey =
list, focused on DS instead of DANE. That is, a rogue zone with =
additional / substitute DS records might affect more than DANE in the =
future.

--Paul Hoffman=

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+1

Paul is right here, the big value in CT is probably applying it as a
reinforcement against people screwing with the DS records or to ensure that
DLV type schemes are not being futzed with.

On Fri, Nov 16, 2012 at 2:06 PM, Paul Hoffman <paul.hoffman@vpnc.org> wrote:

> On Nov 16, 2012, at 3:23 AM, Ben Laurie <benl@google.com> wrote:
>
> > As for CT vs DANE, it is precisely because DNS does not provide a
> > robust infrastructure that DANE cannot be allowed to override CT. This
> > can be fixed by making DANE use some kind of equivalently strong
> > transparency. I agree with others that this is probably better applied
> > to DS records than to TLSA records.
>
> Proposal: we take this off the DANE list and keep it on therightkey list,
> focused on DS instead of DANE. That is, a rogue zone with additional /
> substitute DS records might affect more than DANE in the future.
>
> --Paul Hoffman
> _______________________________________________
> therightkey mailing list
> therightkey@ietf.org
> https://www.ietf.org/mailman/listinfo/therightkey
>



-- 
Website: http://hallambaker.com/

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+1<div><br></div><div>Paul is right here, the big value in CT is probably a=
pplying it as a reinforcement against people screwing with the DS records o=
r to ensure that DLV type schemes are not being futzed with.=A0<br><br><div=
 class=3D"gmail_quote">
On Fri, Nov 16, 2012 at 2:06 PM, Paul Hoffman <span dir=3D"ltr">&lt;<a href=
=3D"mailto:paul.hoffman@vpnc.org" target=3D"_blank">paul.hoffman@vpnc.org</=
a>&gt;</span> wrote:<br><blockquote class=3D"gmail_quote" style=3D"margin:0=
 0 0 .8ex;border-left:1px #ccc solid;padding-left:1ex">
<div class=3D"im">On Nov 16, 2012, at 3:23 AM, Ben Laurie &lt;<a href=3D"ma=
ilto:benl@google.com">benl@google.com</a>&gt; wrote:<br>
<br>
&gt; As for CT vs DANE, it is precisely because DNS does not provide a<br>
&gt; robust infrastructure that DANE cannot be allowed to override CT. This=
<br>
&gt; can be fixed by making DANE use some kind of equivalently strong<br>
&gt; transparency. I agree with others that this is probably better applied=
<br>
&gt; to DS records than to TLSA records.<br>
<br>
</div>Proposal: we take this off the DANE list and keep it on therightkey l=
ist, focused on DS instead of DANE. That is, a rogue zone with additional /=
 substitute DS records might affect more than DANE in the future.<br>
<span class=3D"HOEnZb"><font color=3D"#888888"><br>
--Paul Hoffman<br>
</font></span><div class=3D"HOEnZb"><div class=3D"h5">_____________________=
__________________________<br>
therightkey mailing list<br>
<a href=3D"mailto:therightkey@ietf.org">therightkey@ietf.org</a><br>
<a href=3D"https://www.ietf.org/mailman/listinfo/therightkey" target=3D"_bl=
ank">https://www.ietf.org/mailman/listinfo/therightkey</a><br>
</div></div></blockquote></div><br><br clear=3D"all"><div><br></div>-- <br>=
Website: <a href=3D"http://hallambaker.com/">http://hallambaker.com/</a><br=
><br>
</div>

--14dae93b63201479e604cea47310--

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Subject: Re: [therightkey] [dane]   DANE and CT
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>>>>> "PH" == Paul Hoffman <paul.hoffman@vpnc.org> writes:

PH> Proposal: we take this off the DANE list and keep it on therightkey
PH> list, focused on DS instead of DANE.

+1  TLSA is only one relevant vector for dnssec attacks.  Any such
discussion should be more general.  And tracking DS RRs feels like
enough to provide tamper evidence, at least.

-JimC
-- 
James Cloos <cloos@jhcloos.com>         OpenPGP: 1024D/ED7DAEA6

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References: <CABrd9SRyv+UerPJBf+gw47nWj3t4ekHRnWsKC0pHcadHV5mvmw@mail.gmail.com> <alpine.LSU.2.00.1211141601220.27013@hermes-1.csi.cam.ac.uk> <CABrd9SQ7mt_DSkVimrJ03K9suXEQzYSc_vZ3qUtGLCiphvRetQ@mail.gmail.com> <alpine.LFD.2.02.1211141124490.4326@bofh.nohats.ca> <CABrd9SSv7vfxOhogGmYSWC8hROyXL_z4TJC8mxNMW-apSg5Y0Q@mail.gmail.com> <alpine.LFD.2.02.1211151501490.17666@bofh.nohats.ca> <CABrd9SQPg+5CJk_Quv3J_kOedd+NeDc2aqregdcbWnZofjb8kg@mail.gmail.com> <70D44D23-477C-44AC-AE5F-7EAB7BFA0207@vpnc.org>
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Cc: therightkey@ietf.org, IETF DANE WG list <dane@ietf.org>
Subject: Re: [therightkey] [dane]  DANE and CT
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On 16 November 2012 19:06, Paul Hoffman <paul.hoffman@vpnc.org> wrote:
> On Nov 16, 2012, at 3:23 AM, Ben Laurie <benl@google.com> wrote:
>
>> As for CT vs DANE, it is precisely because DNS does not provide a
>> robust infrastructure that DANE cannot be allowed to override CT. This
>> can be fixed by making DANE use some kind of equivalently strong
>> transparency. I agree with others that this is probably better applied
>> to DS records than to TLSA records.
>
> Proposal: we take this off the DANE list and keep it on therightkey list, focused on DS instead of DANE. That is, a rogue zone with additional / substitute DS records might affect more than DANE in the future.

+1

>
> --Paul Hoffman

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Subject: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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CT-for-PKIX helps a web site administrator determine if a trusted CA =
ever issued a certificate that should not have been issued. =20

CT-for-DNSSEC helps a DNS zone administrator determine whether a DNS =
server in the hierarchy above the leaf zone ever included a DS record =
that should not have been included.

It would be good to have agreement on the above; feel free to offer =
changes and see if the authors agree. Then we can talk about the =
relationship between the two.

--Paul Hoffman=

From shuque@upenn.edu  Sat Nov 17 10:18:42 2012
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From: Shumon Huque <shuque@upenn.edu>
To: Paul Hoffman <paul.hoffman@vpnc.org>
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Subject: Re: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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On Sat, Nov 17, 2012 at 08:01:10AM -0800, Paul Hoffman wrote:
> CT-for-PKIX helps a web site administrator determine if a trusted CA ever issued a certificate that should not have been issued.  
> 
> CT-for-DNSSEC helps a DNS zone administrator determine whether a DNS server in the hierarchy above the leaf zone ever included a DS record that should not have been included.
> 
> It would be good to have agreement on the above; feel free to offer changes and see if the authors agree. Then we can talk about the relationship between the two.
> 

Sounds reasonable to me.

Does "CT" need to be renamed for DNSSEC? Since we're talking about 
transparency of delegation records/keys and not X.509 certificates. 
If C means "certification" in the general sense, then I suppose it
might still be applicable since a (signed) DS record certifies the
authenticity of the secure entry point key in a subordinate zone.

-- 
Shumon Huque
University of Pennsylvania.

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>> CT-for-PKIX helps a web site administrator determine if a trusted CA =
ever issued a certificate that should not have been issued. =20
>>=20
>> CT-for-DNSSEC helps a DNS zone administrator determine whether a DNS =
server in the hierarchy above the leaf zone ever included a DS record =
that should not have been included.
>>=20
>> It would be good to have agreement on the above; feel free to offer =
changes and see if the authors agree. Then we can talk about the =
relationship between the two.
>>=20
>=20
> Sounds reasonable to me.
>=20
> Does "CT" need to be renamed for DNSSEC? Since we're talking about=20
> transparency of delegation records/keys and not X.509 certificates.=20
> If C means "certification" in the general sense, then I suppose it
> might still be applicable since a (signed) DS record certifies the
> authenticity of the secure entry point key in a subordinate zone.

"DST"?

The definitions sound reasonable, but I'm at a loss as to why you would =
bother with "CT-for-DNSSEC".  The whole point of CT is that the space of =
X.509 issuers is very large, and the certificates can be presented by =
any server on the Internet.    It's a hassle to check every, say, HTTPS =
server on the Internet to see if a cert with your name is being =
provided.

In DNSSEC, the set of "issuers" is very small (parent domains), and the =
DS records originate from a well-defined set of sources (authoritative =
servers for those domains).  Checking those servers is not that much =
more difficult than checking a CT log, and doesn't require any new =
protocol.=

From paul.hoffman@vpnc.org  Sat Nov 17 11:37:49 2012
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On Nov 17, 2012, at 11:32 AM, "Richard L. Barnes" <rbarnes@bbn.com> =
wrote:

>>> CT-for-PKIX helps a web site administrator determine if a trusted CA =
ever issued a certificate that should not have been issued. =20
>>>=20
>>> CT-for-DNSSEC helps a DNS zone administrator determine whether a DNS =
server in the hierarchy above the leaf zone ever included a DS record =
that should not have been included.
>>>=20
>>> It would be good to have agreement on the above; feel free to offer =
changes and see if the authors agree. Then we can talk about the =
relationship between the two.
>>>=20
>>=20
>> Sounds reasonable to me.
>>=20
>> Does "CT" need to be renamed for DNSSEC? Since we're talking about=20
>> transparency of delegation records/keys and not X.509 certificates.=20=

>> If C means "certification" in the general sense, then I suppose it
>> might still be applicable since a (signed) DS record certifies the
>> authenticity of the secure entry point key in a subordinate zone.
>=20
> "DST"?
>=20
> The definitions sound reasonable, but I'm at a loss as to why you =
would bother with "CT-for-DNSSEC".  The whole point of CT is that the =
space of X.509 issuers is very large, and the certificates can be =
presented by any server on the Internet.    It's a hassle to check =
every, say, HTTPS server on the Internet to see if a cert with your name =
is being provided.
>=20
> In DNSSEC, the set of "issuers" is very small (parent domains), and =
the DS records originate from a well-defined set of sources =
(authoritative servers for those domains).  Checking those servers is =
not that much more difficult than checking a CT log, and doesn't require =
any new protocol.

Maybe you missed the earlier discussion of this in the past few days.

Rogue DS records might not be detectable to the party with the leaf =
record. For example, assume the domain name example.newtld. The owner of =
example has put DS record A in the newtld zone. If the owner of newtld =
goes rogue and shows DS record B to a limited number of requests (such =
as to a particular geographic region or set of network addresses), the =
party with the private key associated with B can spoof example, and the =
owner of example would not know unless he could see B.

--Paul Hoffman=

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From: Carl Wallace <carl@redhoundsoftware.com>
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Subject: Re: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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On 11/17/12 2:37 PM, "Paul Hoffman" <paul.hoffman@vpnc.org> wrote:

>On Nov 17, 2012, at 11:32 AM, "Richard L. Barnes" <rbarnes@bbn.com> wrote:
>
>>>> CT-for-PKIX helps a web site administrator determine if a trusted CA
>>>>ever issued a certificate that should not have been issued.
>>>> 
>>>> CT-for-DNSSEC helps a DNS zone administrator determine whether a DNS
>>>>server in the hierarchy above the leaf zone ever included a DS record
>>>>that should not have been included.
>>>> 
>>>> It would be good to have agreement on the above; feel free to offer
>>>>changes and see if the authors agree. Then we can talk about the
>>>>relationship between the two.
>>>> 
>>> 
>>> Sounds reasonable to me.
>>> 
>>> Does "CT" need to be renamed for DNSSEC? Since we're talking about
>>> transparency of delegation records/keys and not X.509 certificates.
>>> If C means "certification" in the general sense, then I suppose it
>>> might still be applicable since a (signed) DS record certifies the
>>> authenticity of the secure entry point key in a subordinate zone.
>> 
>> "DST"?
>> 
>> The definitions sound reasonable, but I'm at a loss as to why you would
>>bother with "CT-for-DNSSEC".  The whole point of CT is that the space of
>>X.509 issuers is very large, and the certificates can be presented by
>>any server on the Internet.    It's a hassle to check every, say, HTTPS
>>server on the Internet to see if a cert with your name is being provided.
>> 
>> In DNSSEC, the set of "issuers" is very small (parent domains), and the
>>DS records originate from a well-defined set of sources (authoritative
>>servers for those domains).  Checking those servers is not that much
>>more difficult than checking a CT log, and doesn't require any new
>>protocol.
>
>Maybe you missed the earlier discussion of this in the past few days.
>
>Rogue DS records might not be detectable to the party with the leaf
>record. For example, assume the domain name example.newtld. The owner of
>example has put DS record A in the newtld zone. If the owner of newtld
>goes rogue and shows DS record B to a limited number of requests (such as
>to a particular geographic region or set of network addresses), the party
>with the private key associated with B can spoof example, and the owner
>of example would not know unless he could see B.

Who is intended to be able to contribute to the log?  It seems like for
this to provide the desired visibility, any client should be able to.  For
CT, at least, I thought this was not to be the case. 



From paul@nohats.ca  Sat Nov 17 15:07:25 2012
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Subject: Re: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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On Sat, 17 Nov 2012, Carl Wallace wrote:

>> Rogue DS records might not be detectable to the party with the leaf
>> record. For example, assume the domain name example.newtld. The owner of
>> example has put DS record A in the newtld zone. If the owner of newtld
>> goes rogue and shows DS record B to a limited number of requests (such as
>> to a particular geographic region or set of network addresses), the party
>> with the private key associated with B can spoof example, and the owner
>> of example would not know unless he could see B.
>
> Who is intended to be able to contribute to the log?  It seems like for
> this to provide the desired visibility, any client should be able to.  For
> CT, at least, I thought this was not to be the case.

How do you authenticate that? You cannot use the DS/DNSKEY for
authentication because then the CT audit log is useless to detect
compromises.

And you cannot say "The CA industry" either, which is the answer for the
CT-PKIX version. If you make CT-DNSSEC go through the CA industry, it
will cost $10/year or more to get in the audit log.

Paul

From paul.hoffman@vpnc.org  Sat Nov 17 17:24:10 2012
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Subject: Re: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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On Nov 17, 2012, at 3:06 PM, Paul Wouters <paul@nohats.ca> wrote:

> On Sat, 17 Nov 2012, Carl Wallace wrote:
>=20
>> Who is intended to be able to contribute to the log?  It seems like =
for
>> this to provide the desired visibility, any client should be able to. =
 For
>> CT, at least, I thought this was not to be the case.
>=20
> How do you authenticate that?

The submission includes the whole DNSSEC chain to the root, similar to =
what it does for CT-for-PKIX.

> You cannot use the DS/DNSKEY for
> authentication because then the CT audit log is useless to detect
> compromises.

The purpose is to detect inclusion of DS keys that are not valid to the =
end host, not to detect "compromise". You have been following this =
mailing list, yes?

> And you cannot say "The CA industry" either, which is the answer for =
the
> CT-PKIX version.

OK, so maybe you haven't been following the mailing list or reading the =
draft. In the CT-for-PKIX proposal, individuals can submit their own =
certificate.

> If you make CT-DNSSEC go through the CA industry, it
> will cost $10/year or more to get in the audit log.

Thank you, Strawman McBogusArg!

--Paul Hoffman=

From carl@redhoundsoftware.com  Sat Nov 17 17:32:48 2012
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On 11/17/12 8:24 PM, "Paul Hoffman" <paul.hoffman@vpnc.org> wrote:

>>And you cannot say "The CA industry" either, which is the answer for the
>> CT-PKIX version.
>
>OK, so maybe you haven't been following the mailing list or reading the
>draft. In the CT-for-PKIX proposal, individuals can submit their own
>certificate.

Under this approach, how does the log come to have certificates that a
legitimate owner would like to be made aware of?  I understand the utility
of including the CT in the certificate and having an individual submit
their certificate (or the CA on their behalf) but locking down a log to
these sorts of inputs would seem to limit their usefulness for detecting
rogue certs.  



From paul@nohats.ca  Sat Nov 17 19:58:37 2012
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Subject: Re: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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On Sat, 17 Nov 2012, Carl Wallace wrote:

>> OK, so maybe you haven't been following the mailing list or reading the
>> draft. In the CT-for-PKIX proposal, individuals can submit their own
>> certificate.
>
> Under this approach, how does the log come to have certificates that a
> legitimate owner would like to be made aware of?  I understand the utility
> of including the CT in the certificate and having an individual submit
> their certificate (or the CA on their behalf) but locking down a log to
> these sorts of inputs would seem to limit their usefulness for detecting
> rogue certs.

But allowing anyone to submit "new" certificates, allows hackers to do
the same. How is this authenticated?

For the TLS cert, the "out of band" was via DNS its the MX record. Which
has in fact reduced the security of the CA vouching system. With DNSSEC,
and compromise there, it means even less.

>From my remote participation, I understood the CT audits were
restricted, and that only CAs could submit entries for the audit log,
which is why when this was mentioned I channeled via jabber about
"security through money", and that I thought this was an invalid approach.
(especially for CT-DNSSEC, as publishing DS records is free, unlike
getting a "recognised" PKIX certificate)

On the lists I now hear anyone can submit, which also raises issues.
Perhaps there are very different thoughts for CT-PKIX-CA versus
CT-PKIX-selfsigned that I'm not aware of.

CT-PKIX addresses an issue where there are 600 roots and you can't
trust all of them (although TLSA solves that too). I'm still unsure
what CT-DNSSEC would solve, as just pulling history from DNS does not
add anything, and I have no idea how to authenticate to the CT-DNSSEC
audit log to start an alternative path of trust, especially if you are
defendining against a rogue root or rogue .com key being used secretly
to sign alternative records, or a compromised DNSSEC private key.

Paul

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Date: Sun, 18 Nov 2012 07:56:17 -0500
From: Carl Wallace <carl@redhoundsoftware.com>
To: Paul Wouters <paul@nohats.ca>
Message-ID: <CCCE43DA.364A9%carl@redhoundsoftware.com>
Thread-Topic: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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Cc: therightkey@ietf.org
Subject: Re: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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On 11/17/12 10:57 PM, "Paul Wouters" <paul@nohats.ca> wrote:

>But allowing anyone to submit "new" certificates, allows hackers to do
>the same. How is this authenticated?

For CT, by chaining to a given set of roots.  



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Cc: therightkey@ietf.org, Carl Wallace <carl@redhoundsoftware.com>
Subject: Re: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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On 18 November 2012 03:57, Paul Wouters <paul@nohats.ca> wrote:
> On Sat, 17 Nov 2012, Carl Wallace wrote:
>
>>> OK, so maybe you haven't been following the mailing list or reading the
>>> draft. In the CT-for-PKIX proposal, individuals can submit their own
>>> certificate.
>>
>>
>> Under this approach, how does the log come to have certificates that a
>> legitimate owner would like to be made aware of?  I understand the utility
>> of including the CT in the certificate and having an individual submit
>> their certificate (or the CA on their behalf) but locking down a log to
>> these sorts of inputs would seem to limit their usefulness for detecting
>> rogue certs.
>
>
> But allowing anyone to submit "new" certificates, allows hackers to do
> the same. How is this authenticated?

Your questions confuse me. Have you read the draft? Or any of the
various informal descriptions?

> For the TLS cert, the "out of band" was via DNS its the MX record. Which
> has in fact reduced the security of the CA vouching system. With DNSSEC,
> and compromise there, it means even less.
>
> From my remote participation, I understood the CT audits were
> restricted, and that only CAs could submit entries for the audit log,
> which is why when this was mentioned I channeled via jabber about
> "security through money", and that I thought this was an invalid approach.
> (especially for CT-DNSSEC, as publishing DS records is free, unlike
> getting a "recognised" PKIX certificate)
>
> On the lists I now hear anyone can submit, which also raises issues.
> Perhaps there are very different thoughts for CT-PKIX-CA versus
> CT-PKIX-selfsigned that I'm not aware of.
>
> CT-PKIX addresses an issue where there are 600 roots and you can't
> trust all of them (although TLSA solves that too). I'm still unsure
> what CT-DNSSEC would solve, as just pulling history from DNS does not
> add anything, and I have no idea how to authenticate to the CT-DNSSEC
> audit log to start an alternative path of trust, especially if you are
> defendining against a rogue root or rogue .com key being used secretly
> to sign alternative records, or a compromised DNSSEC private key.
>
> Paul
>
> _______________________________________________
> therightkey mailing list
> therightkey@ietf.org
> https://www.ietf.org/mailman/listinfo/therightkey

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Cc: therightkey@ietf.org, Paul Wouters <paul@nohats.ca>, Paul Hoffman <paul.hoffman@vpnc.org>
Subject: Re: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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On 18 November 2012 01:32, Carl Wallace <carl@redhoundsoftware.com> wrote:
> On 11/17/12 8:24 PM, "Paul Hoffman" <paul.hoffman@vpnc.org> wrote:
>
>>>And you cannot say "The CA industry" either, which is the answer for the
>>> CT-PKIX version.
>>
>>OK, so maybe you haven't been following the mailing list or reading the
>>draft. In the CT-for-PKIX proposal, individuals can submit their own
>>certificate.
>
> Under this approach, how does the log come to have certificates that a
> legitimate owner would like to be made aware of?  I understand the utility
> of including the CT in the certificate and having an individual submit
> their certificate (or the CA on their behalf) but locking down a log to
> these sorts of inputs would seem to limit their usefulness for detecting
> rogue certs.

The idea is that the log contains all certificates the browser might
otherwise say are valid. If the cert would not be validated by the
browser anyway, there's no real point it being in the log - and so,
for pragmatic reasons (i.e. spam prevention), our current plan is to
not allow such certificates to be logged.

From carl@redhoundsoftware.com  Mon Nov 19 04:08:20 2012
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Date: Mon, 19 Nov 2012 06:49:28 -0500
From: Carl Wallace <carl@redhoundsoftware.com>
To: Ben Laurie <benl@google.com>
Message-ID: <CCCF8519.364EA%carl@redhoundsoftware.com>
Thread-Topic: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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Cc: therightkey@ietf.org, Paul Wouters <paul@nohats.ca>, Paul Hoffman <paul.hoffman@vpnc.org>
Subject: Re: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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On 11/19/12 5:30 AM, "Ben Laurie" <benl@google.com> wrote:

>On 18 November 2012 01:32, Carl Wallace <carl@redhoundsoftware.com> wrote:
>> On 11/17/12 8:24 PM, "Paul Hoffman" <paul.hoffman@vpnc.org> wrote:
>>
>>>>And you cannot say "The CA industry" either, which is the answer for
>>>>the
>>>> CT-PKIX version.
>>>
>>>OK, so maybe you haven't been following the mailing list or reading the
>>>draft. In the CT-for-PKIX proposal, individuals can submit their own
>>>certificate.
>>
>> Under this approach, how does the log come to have certificates that a
>> legitimate owner would like to be made aware of?  I understand the
>>utility
>> of including the CT in the certificate and having an individual submit
>> their certificate (or the CA on their behalf) but locking down a log to
>> these sorts of inputs would seem to limit their usefulness for detecting
>> rogue certs.
>
>The idea is that the log contains all certificates the browser might
>otherwise say are valid. If the cert would not be validated by the
>browser anyway, there's no real point it being in the log - and so,
>for pragmatic reasons (i.e. spam prevention), our current plan is to
>not allow such certificates to be logged.

That is only true for browsers that hard fail on missing/broken CT
extensions.  I've not followed why hard failing on this is expected to
work but not for other existing mechanisms.  We still have 15+ year olds
extensions that don't cause hard failures.  Pushing the extension into the
certificate and only accepting certs that have it just makes this part of
the issuance machinery.

In any case, I have a hard time seeing why you would reject certificates
signed by a public CA (or any other CA that is covered by the log).  CA
operators and legitimate domain owners should be interested in these and
the signature check ought to be good enough for spam prevention unless
things are more broken than is commonly reported.        



From benl@google.com  Mon Nov 19 05:08:24 2012
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Subject: Re: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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On 19 November 2012 11:49, Carl Wallace <carl@redhoundsoftware.com> wrote:
> On 11/19/12 5:30 AM, "Ben Laurie" <benl@google.com> wrote:
>
>>On 18 November 2012 01:32, Carl Wallace <carl@redhoundsoftware.com> wrote:
>>> On 11/17/12 8:24 PM, "Paul Hoffman" <paul.hoffman@vpnc.org> wrote:
>>>
>>>>>And you cannot say "The CA industry" either, which is the answer for
>>>>>the
>>>>> CT-PKIX version.
>>>>
>>>>OK, so maybe you haven't been following the mailing list or reading the
>>>>draft. In the CT-for-PKIX proposal, individuals can submit their own
>>>>certificate.
>>>
>>> Under this approach, how does the log come to have certificates that a
>>> legitimate owner would like to be made aware of?  I understand the
>>>utility
>>> of including the CT in the certificate and having an individual submit
>>> their certificate (or the CA on their behalf) but locking down a log to
>>> these sorts of inputs would seem to limit their usefulness for detecting
>>> rogue certs.
>>
>>The idea is that the log contains all certificates the browser might
>>otherwise say are valid. If the cert would not be validated by the
>>browser anyway, there's no real point it being in the log - and so,
>>for pragmatic reasons (i.e. spam prevention), our current plan is to
>>not allow such certificates to be logged.
>
> That is only true for browsers that hard fail on missing/broken CT
> extensions.

What is only true? That there's no point it being in the log if the
browser would reject it anyway? I don't understand that.

> I've not followed why hard failing on this is expected to
> work but not for other existing mechanisms.  We still have 15+ year olds
> extensions that don't cause hard failures.  Pushing the extension into the
> certificate and only accepting certs that have it just makes this part of
> the issuance machinery.

The extension does not have to be in the certificate, it can also be
in the TLS handshake.

> In any case, I have a hard time seeing why you would reject certificates
> signed by a public CA (or any other CA that is covered by the log).  CA
> operators and legitimate domain owners should be interested in these and
> the signature check ought to be good enough for spam prevention unless
> things are more broken than is commonly reported.

We would not reject them. Why do you think we would?

From carl@redhoundsoftware.com  Mon Nov 19 05:20:51 2012
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Date: Mon, 19 Nov 2012 08:20:42 -0500
From: Carl Wallace <carl@redhoundsoftware.com>
To: Ben Laurie <benl@google.com>
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Thread-Topic: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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On 11/19/12 8:08 AM, "Ben Laurie" <benl@google.com> wrote:
>> In any case, I have a hard time seeing why you would reject certificates
>> signed by a public CA (or any other CA that is covered by the log).  CA
>> operators and legitimate domain owners should be interested in these and
>> the signature check ought to be good enough for spam prevention unless
>> things are more broken than is commonly reported.
>
>We would not reject them. Why do you think we would?

A misunderstanding I hope.  If you are saying that browsers/observers
can/would submit certificates that chain through a CA covered by the log
then I have no issue.  If (as I had come to think) the log is fed during
issuance, then I think a significant part of the potential value is lost.

Part of the problem in tracking this right now is the TBD in section 3 of
the draft.  I'll refrain from further comment until that text is present,
since that should clarify things.    



From benl@google.com  Mon Nov 19 05:34:17 2012
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On 19 November 2012 13:20, Carl Wallace <carl@redhoundsoftware.com> wrote:
> On 11/19/12 8:08 AM, "Ben Laurie" <benl@google.com> wrote:
>>> In any case, I have a hard time seeing why you would reject certificates
>>> signed by a public CA (or any other CA that is covered by the log).  CA
>>> operators and legitimate domain owners should be interested in these and
>>> the signature check ought to be good enough for spam prevention unless
>>> things are more broken than is commonly reported.
>>
>>We would not reject them. Why do you think we would?
>
> A misunderstanding I hope.  If you are saying that browsers/observers
> can/would submit certificates that chain through a CA covered by the log
> then I have no issue.  If (as I had come to think) the log is fed during
> issuance, then I think a significant part of the potential value is lost.

Anyone can submit to the log. The log (at least our log!) will accept
any certificate chained through a public CA.

> Part of the problem in tracking this right now is the TBD in section 3 of
> the draft.  I'll refrain from further comment until that text is present,
> since that should clarify things.

I will at least outline what will be in the messages soon.

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Subject: [therightkey] What next for CT?
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Dear Group,

Following the recent BoF and discussion with Stephen Farrell, the plan
is to try to publish an experimental RFC for CT and, all going well,
follow up later with a WG.

In the experimental RFC we will cover the operation of the log, the
log protocol and TLS client verification of CT. We will be
specifically targetting the use of CT with PKI for HTTPS, and not
other applications such as DNSSEC, self-signed certs, device certs,
other TLS secured protocols, etc. Not that we exclude the possibility
of using transparency logs for such things, of course, they just will
not be covered by this initial RFC.

The RFC will be broadly similar the existing I-D but will flesh out
the protocols for interacting with the log, as far as they are
currently defined. It will add RSA signatures for logs that would
prefer to use it.

It will not cover details of the audit process (that is, how clients
verify that the timestamps they see really are included in the public
log) as we think that will evolve quite rapidly for some time to come.

The approximate timeline is that we hope to go to IETF last call
around the end of the year.

I intend to put out at least one more version for comment before that,
though.

As always, all comments are welcome.

Cheers,

Ben.

From hallam@gmail.com  Tue Nov 20 05:03:33 2012
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From: Phillip Hallam-Baker <hallam@gmail.com>
To: Ben Laurie <benl@google.com>
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Subject: Re: [therightkey] What next for CT?
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I think there should be two separate drafts.

1) Cover the technical spec describing how the notary log system works, the
data formats etc.
2) Cover the use of the scheme in the context of PKIX.

(1) is then reusable to other applications.

Phill

On Tue, Nov 20, 2012 at 7:33 AM, Ben Laurie <benl@google.com> wrote:

> Dear Group,
>
> Following the recent BoF and discussion with Stephen Farrell, the plan
> is to try to publish an experimental RFC for CT and, all going well,
> follow up later with a WG.
>
> In the experimental RFC we will cover the operation of the log, the
> log protocol and TLS client verification of CT. We will be
> specifically targetting the use of CT with PKI for HTTPS, and not
> other applications such as DNSSEC, self-signed certs, device certs,
> other TLS secured protocols, etc. Not that we exclude the possibility
> of using transparency logs for such things, of course, they just will
> not be covered by this initial RFC.
>
> The RFC will be broadly similar the existing I-D but will flesh out
> the protocols for interacting with the log, as far as they are
> currently defined. It will add RSA signatures for logs that would
> prefer to use it.
>
> It will not cover details of the audit process (that is, how clients
> verify that the timestamps they see really are included in the public
> log) as we think that will evolve quite rapidly for some time to come.
>
> The approximate timeline is that we hope to go to IETF last call
> around the end of the year.
>
> I intend to put out at least one more version for comment before that,
> though.
>
> As always, all comments are welcome.
>
> Cheers,
>
> Ben.
> _______________________________________________
> therightkey mailing list
> therightkey@ietf.org
> https://www.ietf.org/mailman/listinfo/therightkey
>



-- 
Website: http://hallambaker.com/

--f46d0447f1886931ca04ceecdc25
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I think there should be two separate drafts.=A0<div><br></div><div>1) Cover=
 the technical spec describing how the notary log system works, the data fo=
rmats etc.</div><div>2) Cover the use of the scheme in the context of PKIX.=
</div>
<div><br></div><div>(1) is then reusable to other applications.=A0</div><di=
v><br></div><div>Phill</div><div><br><div class=3D"gmail_quote">On Tue, Nov=
 20, 2012 at 7:33 AM, Ben Laurie <span dir=3D"ltr">&lt;<a href=3D"mailto:be=
nl@google.com" target=3D"_blank">benl@google.com</a>&gt;</span> wrote:<br>
<blockquote class=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1p=
x #ccc solid;padding-left:1ex">Dear Group,<br>
<br>
Following the recent BoF and discussion with Stephen Farrell, the plan<br>
is to try to publish an experimental RFC for CT and, all going well,<br>
follow up later with a WG.<br>
<br>
In the experimental RFC we will cover the operation of the log, the<br>
log protocol and TLS client verification of CT. We will be<br>
specifically targetting the use of CT with PKI for HTTPS, and not<br>
other applications such as DNSSEC, self-signed certs, device certs,<br>
other TLS secured protocols, etc. Not that we exclude the possibility<br>
of using transparency logs for such things, of course, they just will<br>
not be covered by this initial RFC.<br>
<br>
The RFC will be broadly similar the existing I-D but will flesh out<br>
the protocols for interacting with the log, as far as they are<br>
currently defined. It will add RSA signatures for logs that would<br>
prefer to use it.<br>
<br>
It will not cover details of the audit process (that is, how clients<br>
verify that the timestamps they see really are included in the public<br>
log) as we think that will evolve quite rapidly for some time to come.<br>
<br>
The approximate timeline is that we hope to go to IETF last call<br>
around the end of the year.<br>
<br>
I intend to put out at least one more version for comment before that,<br>
though.<br>
<br>
As always, all comments are welcome.<br>
<br>
Cheers,<br>
<br>
Ben.<br>
_______________________________________________<br>
therightkey mailing list<br>
<a href=3D"mailto:therightkey@ietf.org">therightkey@ietf.org</a><br>
<a href=3D"https://www.ietf.org/mailman/listinfo/therightkey" target=3D"_bl=
ank">https://www.ietf.org/mailman/listinfo/therightkey</a><br>
</blockquote></div><br><br clear=3D"all"><div><br></div>-- <br>Website: <a =
href=3D"http://hallambaker.com/">http://hallambaker.com/</a><br><br>
</div>

--f46d0447f1886931ca04ceecdc25--

From stephen.farrell@cs.tcd.ie  Tue Nov 20 05:07:37 2012
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Cc: therightkey@ietf.org, Ben Laurie <benl@google.com>
Subject: Re: [therightkey] What next for CT?
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Hi Phill,

Not sure what Ben thinks of that but I'd rather
just AD sponsor one draft for now. A split like
that would definitely make sense for the
standards-track work that's envisaged to follow
though. Do you think that's really a must-have
at this stage? I guess I don't, as of now.

Cheers,
S.

On 11/20/2012 01:03 PM, Phillip Hallam-Baker wrote:
> I think there should be two separate drafts.
> 
> 1) Cover the technical spec describing how the notary log system works, the
> data formats etc.
> 2) Cover the use of the scheme in the context of PKIX.
> 
> (1) is then reusable to other applications.
> 
> Phill
> 
> On Tue, Nov 20, 2012 at 7:33 AM, Ben Laurie <benl@google.com> wrote:
> 
>> Dear Group,
>>
>> Following the recent BoF and discussion with Stephen Farrell, the plan
>> is to try to publish an experimental RFC for CT and, all going well,
>> follow up later with a WG.
>>
>> In the experimental RFC we will cover the operation of the log, the
>> log protocol and TLS client verification of CT. We will be
>> specifically targetting the use of CT with PKI for HTTPS, and not
>> other applications such as DNSSEC, self-signed certs, device certs,
>> other TLS secured protocols, etc. Not that we exclude the possibility
>> of using transparency logs for such things, of course, they just will
>> not be covered by this initial RFC.
>>
>> The RFC will be broadly similar the existing I-D but will flesh out
>> the protocols for interacting with the log, as far as they are
>> currently defined. It will add RSA signatures for logs that would
>> prefer to use it.
>>
>> It will not cover details of the audit process (that is, how clients
>> verify that the timestamps they see really are included in the public
>> log) as we think that will evolve quite rapidly for some time to come.
>>
>> The approximate timeline is that we hope to go to IETF last call
>> around the end of the year.
>>
>> I intend to put out at least one more version for comment before that,
>> though.
>>
>> As always, all comments are welcome.
>>
>> Cheers,
>>
>> Ben.
>> _______________________________________________
>> therightkey mailing list
>> therightkey@ietf.org
>> https://www.ietf.org/mailman/listinfo/therightkey
>>
> 
> 
> 
> 
> 
> _______________________________________________
> therightkey mailing list
> therightkey@ietf.org
> https://www.ietf.org/mailman/listinfo/therightkey
> 

From benl@google.com  Tue Nov 20 05:14:31 2012
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Subject: Re: [therightkey] What next for CT?
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On 20 November 2012 13:07, Stephen Farrell <stephen.farrell@cs.tcd.ie> wrote:
>
> Hi Phill,
>
> Not sure what Ben thinks of that but I'd rather
> just AD sponsor one draft for now. A split like
> that would definitely make sense for the
> standards-track work that's envisaged to follow
> though. Do you think that's really a must-have
> at this stage? I guess I don't, as of now.

My view is that teasing the two parts apart is hard and so I agree it
would be good for standards track, but don't want to do it for
experimental.

>
> Cheers,
> S.
>
> On 11/20/2012 01:03 PM, Phillip Hallam-Baker wrote:
>> I think there should be two separate drafts.
>>
>> 1) Cover the technical spec describing how the notary log system works, the
>> data formats etc.
>> 2) Cover the use of the scheme in the context of PKIX.
>>
>> (1) is then reusable to other applications.
>>
>> Phill
>>
>> On Tue, Nov 20, 2012 at 7:33 AM, Ben Laurie <benl@google.com> wrote:
>>
>>> Dear Group,
>>>
>>> Following the recent BoF and discussion with Stephen Farrell, the plan
>>> is to try to publish an experimental RFC for CT and, all going well,
>>> follow up later with a WG.
>>>
>>> In the experimental RFC we will cover the operation of the log, the
>>> log protocol and TLS client verification of CT. We will be
>>> specifically targetting the use of CT with PKI for HTTPS, and not
>>> other applications such as DNSSEC, self-signed certs, device certs,
>>> other TLS secured protocols, etc. Not that we exclude the possibility
>>> of using transparency logs for such things, of course, they just will
>>> not be covered by this initial RFC.
>>>
>>> The RFC will be broadly similar the existing I-D but will flesh out
>>> the protocols for interacting with the log, as far as they are
>>> currently defined. It will add RSA signatures for logs that would
>>> prefer to use it.
>>>
>>> It will not cover details of the audit process (that is, how clients
>>> verify that the timestamps they see really are included in the public
>>> log) as we think that will evolve quite rapidly for some time to come.
>>>
>>> The approximate timeline is that we hope to go to IETF last call
>>> around the end of the year.
>>>
>>> I intend to put out at least one more version for comment before that,
>>> though.
>>>
>>> As always, all comments are welcome.
>>>
>>> Cheers,
>>>
>>> Ben.
>>> _______________________________________________
>>> therightkey mailing list
>>> therightkey@ietf.org
>>> https://www.ietf.org/mailman/listinfo/therightkey
>>>
>>
>>
>>
>>
>>
>> _______________________________________________
>> therightkey mailing list
>> therightkey@ietf.org
>> https://www.ietf.org/mailman/listinfo/therightkey
>>

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Subject: Re: [therightkey] What next for CT?
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On Tue, Nov 20, 2012 at 8:14 AM, Ben Laurie <benl@google.com> wrote:

> On 20 November 2012 13:07, Stephen Farrell <stephen.farrell@cs.tcd.ie>
> wrote:
> >
> > Hi Phill,
> >
> > Not sure what Ben thinks of that but I'd rather
> > just AD sponsor one draft for now. A split like
> > that would definitely make sense for the
> > standards-track work that's envisaged to follow
> > though. Do you think that's really a must-have
> > at this stage? I guess I don't, as of now.
>
> My view is that teasing the two parts apart is hard and so I agree it
> would be good for standards track, but don't want to do it for
> experimental.


My objective was to get the two parts teased apart rather than the
presentation as separate documents.

I think the exercise would improve the clarity of the spec.

-- 
Website: http://hallambaker.com/

--e89a8fb1f418f6c19504ceed0d93
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On Tue, Nov 20, 2012 at 8:14 AM, Ben Laurie <span dir=3D"ltr">&lt;<a href=
=3D"mailto:benl@google.com" target=3D"_blank">benl@google.com</a>&gt;</span=
> wrote:<br><div class=3D"gmail_quote"><blockquote class=3D"gmail_quote" st=
yle=3D"margin:0 0 0 .8ex;border-left:1px #ccc solid;padding-left:1ex">
<div class=3D"im">On 20 November 2012 13:07, Stephen Farrell &lt;<a href=3D=
"mailto:stephen.farrell@cs.tcd.ie">stephen.farrell@cs.tcd.ie</a>&gt; wrote:=
<br>
&gt;<br>
&gt; Hi Phill,<br>
&gt;<br>
&gt; Not sure what Ben thinks of that but I&#39;d rather<br>
&gt; just AD sponsor one draft for now. A split like<br>
&gt; that would definitely make sense for the<br>
&gt; standards-track work that&#39;s envisaged to follow<br>
&gt; though. Do you think that&#39;s really a must-have<br>
&gt; at this stage? I guess I don&#39;t, as of now.<br>
<br>
</div>My view is that teasing the two parts apart is hard and so I agree it=
<br>
would be good for standards track, but don&#39;t want to do it for<br>
experimental.</blockquote><div><br></div><div>My objective was to get the t=
wo parts teased apart rather than the presentation as separate documents.</=
div><div><br></div><div>I think the exercise would improve the clarity of t=
he spec.</div>
<div>=A0</div></div>-- <br>Website: <a href=3D"http://hallambaker.com/">htt=
p://hallambaker.com/</a><br><br>

--e89a8fb1f418f6c19504ceed0d93--

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Subject: Re: [therightkey] What next for CT?
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On 20 November 2012 13:17, Phillip Hallam-Baker <hallam@gmail.com> wrote:
> On Tue, Nov 20, 2012 at 8:14 AM, Ben Laurie <benl@google.com> wrote:
>>
>> On 20 November 2012 13:07, Stephen Farrell <stephen.farrell@cs.tcd.ie>
>> wrote:
>> >
>> > Hi Phill,
>> >
>> > Not sure what Ben thinks of that but I'd rather
>> > just AD sponsor one draft for now. A split like
>> > that would definitely make sense for the
>> > standards-track work that's envisaged to follow
>> > though. Do you think that's really a must-have
>> > at this stage? I guess I don't, as of now.
>>
>> My view is that teasing the two parts apart is hard and so I agree it
>> would be good for standards track, but don't want to do it for
>> experimental.
>
>
> My objective was to get the two parts teased apart rather than the
> presentation as separate documents.
>
> I think the exercise would improve the clarity of the spec.

Its still hard :-)

I'll see what I can do, though.

From tom@ritter.vg  Tue Nov 20 15:47:32 2012
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From: Tom Ritter <tom@ritter.vg>
Date: Tue, 20 Nov 2012 18:47:09 -0500
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Subject: Re: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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--20cf307f362c6eec8704cef5db20
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On 17 November 2012 22:57, Paul Wouters <paul@nohats.ca> wrote:

> CT-PKIX addresses an issue where there are 600 roots and you can't
> trust all of them (although TLSA solves that too). I'm still unsure
> what CT-DNSSEC would solve, as just pulling history from DNS does not
> add anything, and I have no idea how to authenticate to the CT-DNSSEC
> audit log to start an alternative path of trust, especially if you are
> defendining against a rogue root or rogue .com key being used secretly
> to sign alternative records, or a compromised DNSSEC private key.


I'd like to state what I think CT-DNSSEC would solve, and how it would
work.  I'll use .com as my example root, and google as my example CT
notary.  Hopefully I don't screw up the DNSSEC part or the CT part too
much...

I submit an entry for the DS record for example.com to the .com operator.
 The operator in turn contacts google but preferably multiple notaries and
says "This is the DS record for example.com" and google puts it into their
log, and gives back a signed statement as proof of such.  It then enters
this proof in some new type of record, we'll call it DSProof.  After the
.com operator has the proof, it updates the DS and DSProof records.

Now a user wants to connect securely to example.com.  They query the A
record for example.com, and get back the response plus the RRSIG, the
signature for the A record.  However, the client can't check the signature,
it doesn't have the key.  I'm unsure if in implementations this query
happens in parallel, in the same query or what - but it reaches out and
gets the ZSK for example.com, the KSK for example.com, and the DS record
for example.com - so it has the complete chain of keys from example.com ->
.com -> (root).  At this point it can verify the entire chain of
signatures.  But when it retrieves the DS record for example.com it also
retrieves the DSProof.

The client can verify that the DSProof is valid and comes from the google
notary (I'm not 100% sure if this is a signature of a merkle path ending in
a signature but it functions like a signature.)  The client ensures that
the DSProof is valid and from the google notary, meaning it has an entry in
the append-only merkel tree, which we can verify (and there
are verifiers for it.)  That gets into the CT side of things.

At this point, everything under example.com - whether it's the A record or
the TLSA record - is signed as normal, and the signatures under
example.comchain to a key that has been entered into a public log.  If
a TLD wants
to fraudulently sign a response for the A or TLSA record for a site, they
will have to also enter the key into the notary.  The operator of
example.com will be able to see there is a DS record they did not authorize
in the notary, and can start investigations or other mitigation processes.
 (Ideally the presence of the notaries will be the deterrent against the
attack.)

I think CT-DNSSEC is important.  We've seen domain seizures before. The new
gTLD program will open the internet to vast numbers of root operators, and
not all of them will be competent or lack malice.  Root keys will get
stolen.  Maybe it'll be .bugatti and not .bank but it will still happen.
 We should build this in now, while we can flesh it out pre-widespread
deployment of DNSSEC.

-tom

--20cf307f362c6eec8704cef5db20
Content-Type: text/html; charset=ISO-8859-1
Content-Transfer-Encoding: quoted-printable

On 17 November 2012 22:57, Paul Wouters <span dir=3D"ltr">&lt;<a href=3D"ma=
ilto:paul@nohats.ca" target=3D"_blank">paul@nohats.ca</a>&gt;</span> wrote:=
<br><div class=3D"gmail_extra"><div class=3D"gmail_quote"><blockquote class=
=3D"gmail_quote" style=3D"margin:0 0 0 .8ex;border-left:1px #ccc solid;padd=
ing-left:1ex">


<div>CT-PKIX addresses an issue where there are 600 roots and you can&#39;t=
<br></div>
trust all of them (although TLSA solves that too). I&#39;m still unsure<br>
what CT-DNSSEC would solve, as just pulling history from DNS does not<br>
add anything, and I have no idea how to authenticate to the CT-DNSSEC<br>
audit log to start an alternative path of trust, especially if you are<br>
defendining against a rogue root or rogue .com key being used secretly<br>
to sign alternative records, or a compromised DNSSEC private key.</blockquo=
te><div><br></div><div>I&#39;d like to state what I think CT-DNSSEC would s=
olve, and how it would work. =A0I&#39;ll use .com as my example root, and g=
oogle as my example CT notary. =A0Hopefully I don&#39;t screw up the DNSSEC=
 part or the CT part too much...</div>


<div><br></div><div>I submit an entry for the DS record for <a href=3D"http=
://example.com" target=3D"_blank">example.com</a> to the .com operator. =A0=
The operator in turn contacts google but=A0preferably=A0multiple notaries a=
nd says &quot;This is the DS record for <a href=3D"http://example.com" targ=
et=3D"_blank">example.com</a>&quot; and google puts it into their log, and =
gives back a signed statement as proof of such. =A0It then enters this proo=
f in some new type of record, we&#39;ll call it DSProof. =A0After the .com =
operator has the proof, it updates the DS and DSProof records.</div>

<div><br></div><div>Now a user wants to connect securely to <a href=3D"http=
://example.com">example.com</a>. =A0They query the A record for <a href=3D"=
http://example.com">example.com</a>, and get back the response plus the RRS=
IG, the signature for the A record. =A0However, the client can&#39;t check =
the signature, it doesn&#39;t have the key. =A0I&#39;m unsure if in impleme=
ntations this query happens in=A0parallel, in the same query or what - but =
it reaches out and gets the ZSK for <a href=3D"http://example.com">example.=
com</a>, the KSK for <a href=3D"http://example.com">example.com</a>, and th=
e DS record for <a href=3D"http://example.com">example.com</a> - so it has =
the complete chain of keys from <a href=3D"http://example.com">example.com<=
/a> -&gt; .com -&gt; (root). =A0At this point it can verify the entire chai=
n of signatures. =A0But when it retrieves the DS record for <a href=3D"http=
://example.com">example.com</a> it also retrieves the DSProof. =A0</div>

<div><br></div><div>The client can verify that the DSProof is valid and com=
es from the google notary (I&#39;m not 100% sure if this is a signature of =
a merkle path ending in a signature but it functions like a signature.) =A0=
The client ensures that the DSProof is valid and from the google notary, me=
aning it has an entry in the=A0append-only merkel tree, which we can verify=
 (and there are=A0verifiers=A0for it.) =A0That gets into the CT side of thi=
ngs.</div>

<div><br></div><div>At this point, everything under <a href=3D"http://examp=
le.com">example.com</a> - whether it&#39;s the A record or the TLSA record =
- is signed as normal, and the signatures under <a href=3D"http://example.c=
om">example.com</a> chain to a key that has been entered into a public log.=
 =A0If a TLD wants to=A0fraudulently=A0sign a response for the A or TLSA re=
cord for a site, they will have to also enter the key into the notary. =A0T=
he operator of <a href=3D"http://example.com">example.com</a> will be able =
to see there is a DS record they did not authorize in the notary, and can s=
tart investigations or other mitigation processes. =A0(Ideally the presence=
 of the notaries will be the deterrent against the attack.)</div>

<div><br></div><div>I think CT-DNSSEC is important. =A0We&#39;ve seen domai=
n seizures before. The new gTLD program will open the internet to vast numb=
ers of root operators, and not all of them will be=A0competent or lack mali=
ce. =A0Root keys will get stolen. =A0Maybe it&#39;ll be .bugatti and not .b=
ank but it will still happen. =A0We should build this in now, while we can =
flesh it out pre-widespread deployment of DNSSEC.</div>

<div><br></div><div>-tom</div>
</div></div>

--20cf307f362c6eec8704cef5db20--

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From: Ben Laurie <benl@google.com>
To: Tom Ritter <tom@ritter.vg>
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Cc: therightkey <therightkey@ietf.org>, Paul Wouters <paul@nohats.ca>, Carl Wallace <carl@redhoundsoftware.com>
Subject: Re: [therightkey] Defining CT-for-PKIX and CT-for-DNSSEC
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On 20 November 2012 23:47, Tom Ritter <tom@ritter.vg> wrote:
> On 17 November 2012 22:57, Paul Wouters <paul@nohats.ca> wrote:
>>
>> CT-PKIX addresses an issue where there are 600 roots and you can't
>> trust all of them (although TLSA solves that too). I'm still unsure
>> what CT-DNSSEC would solve, as just pulling history from DNS does not
>> add anything, and I have no idea how to authenticate to the CT-DNSSEC
>> audit log to start an alternative path of trust, especially if you are
>> defendining against a rogue root or rogue .com key being used secretly
>> to sign alternative records, or a compromised DNSSEC private key.
>
>
> I'd like to state what I think CT-DNSSEC would solve, and how it would work.
> I'll use .com as my example root, and google as my example CT notary.
> Hopefully I don't screw up the DNSSEC part or the CT part too much...

This looks about right to me, just one clarification. Also, as others
have said, CT-DNSSEC is probably not the right name for it!

> I submit an entry for the DS record for example.com to the .com operator.
> The operator in turn contacts google but preferably multiple notaries and
> says "This is the DS record for example.com" and google puts it into their
> log, and gives back a signed statement as proof of such.  It then enters
> this proof in some new type of record, we'll call it DSProof.  After the
> .com operator has the proof, it updates the DS and DSProof records.
>
> Now a user wants to connect securely to example.com.  They query the A
> record for example.com, and get back the response plus the RRSIG, the
> signature for the A record.  However, the client can't check the signature,
> it doesn't have the key.  I'm unsure if in implementations this query
> happens in parallel, in the same query or what - but it reaches out and gets
> the ZSK for example.com, the KSK for example.com, and the DS record for
> example.com - so it has the complete chain of keys from example.com -> .com
> -> (root).  At this point it can verify the entire chain of signatures.  But
> when it retrieves the DS record for example.com it also retrieves the
> DSProof.
>
> The client can verify that the DSProof is valid and comes from the google
> notary (I'm not 100% sure if this is a signature of a merkle path ending in
> a signature but it functions like a signature.)

In CT this is a signature from the log that is in effect a promise to
include the cert in the log. This is so that the CT log server can
respond immediately to a certificate request without having to
generate a whole new tree. We did this in the interest of reliability
and uptime (since there can only be one correct tree, it is required
that all responses from a server farm are ordered, which is
considerably more demanding than it is to store certificates for later
ordering, in short).

However, if DNSSEC servers are prepared to wait a while, sometimes,
then we could make it an actual merkle path - this was the original
design of CT, but CAs didn't like the delay.

>  The client ensures that the
> DSProof is valid and from the google notary, meaning it has an entry in the
> append-only merkel tree, which we can verify (and there are verifiers for
> it.)  That gets into the CT side of things.
>
> At this point, everything under example.com - whether it's the A record or
> the TLSA record - is signed as normal, and the signatures under example.com
> chain to a key that has been entered into a public log.  If a TLD wants to
> fraudulently sign a response for the A or TLSA record for a site, they will
> have to also enter the key into the notary.  The operator of example.com
> will be able to see there is a DS record they did not authorize in the
> notary, and can start investigations or other mitigation processes.
> (Ideally the presence of the notaries will be the deterrent against the
> attack.)
>
> I think CT-DNSSEC is important.  We've seen domain seizures before. The new
> gTLD program will open the internet to vast numbers of root operators, and
> not all of them will be competent or lack malice.  Root keys will get
> stolen.  Maybe it'll be .bugatti and not .bank but it will still happen.  We
> should build this in now, while we can flesh it out pre-widespread
> deployment of DNSSEC.
>
> -tom
>
> _______________________________________________
> therightkey mailing list
> therightkey@ietf.org
> https://www.ietf.org/mailman/listinfo/therightkey
>

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Subject: [therightkey] Comments on Draft
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In the current draft, there may be some minor errors in the description of =
the algorithms or confusion on my side on the nature of the notation.

The notation would be much clearer if the merkle tree nodes were indexed by=
 the tuple representing the range of the hashed values covered by the node.

I've attached below an alternate description of the trees showing the corre=
spondence of the nodes to the range tuple and a short summary of the algori=
thms using this notation.

Paul

PS - will publish associated Python code eventually

   =20
           0,3              0,4
          __|__            __|__=20
         /     \          /     \
       0,2     2,3      0,2     2,4
      /   \     |       / \     / \
    0,1   1,2  d2     0,1 1,2 2,3 3,4
     |     |           |   |   |   |
    d0    d1          d0  d1  d2  d3=20
 =20
   Each hash in the tree can be identified as a tuple representing the rang=
e
   of values covered by the hash.
  =20
   For a Merkle Hash Tree with n leaf nodes and each i,j node
   identified by mth(i,j):
    - the root hash, MTH =3D mth(0,n)
    - the leaf hash for data entry di with 0<=3Di<n is mth(i,i+1)
    - leaf values are formed by hashing the input string d(i)
        mth(i,i+1) =3D hash( 0 | d(i))
        This is a hash of the single octet with value 0 concatenated with
        the ith input string d(i)
    - every non-leaf node mth(k1,k2) has the property that
        mth(k1,k2) =3D hash( 1 | mth(k1,k) | mth(k,k2) )
        where k =3D k1+lp2(k2-k1) , and lp2(i) is the largest power of 2 < =
i
    - new entries are added to the tree by:
      creating a leaf node
        mth(i,i+1) =3D hash( 0 | d(i))
      creating a new root hash
        mth(0,i+1) =3D hash( 1 + mth(k1,k) | mth(k,k2))
      recursively creating any mth(i,j) needed for the new root hash
    - an empty tree has a root hash value formed by hashing
      a null string, hash('')
     =20
   For n > 1, the audit path for the (m+1)th element d(m) in a list=20
   of n > m elements is found by the recursive function: =20
  =20
   PATH(m, D[0:n])

   Where:

   PATH(m, D[k1,k2]) =3D {} for (k2-k1)=3D1

   k =3D k1 + largestPower2(k2-k1)
  =20
   PATH(m, D[k1:k2]) =3D PATH(m, D[k1:k]) : MTH(D[k:k2]) for m < k; and
  =20
   PATH(m, D[k1:k2]) =3D PATH(m, D[k:k2]) : MTH(D[k1:k]) for m >=3D k,

                  0,7
             ______|______
            /             \  =20
          0,4             4,7          =20
         __|__           __|__
        /     \         /     \
      0,2     2,4     4,6     6,7
      / \     / \     / \      |
    0,1 1,2 2,3 3,4 4,5 5,6   d6
     |   |   |   |   |   |
    d0  d1  d2  d3  d4  d5 =20
  =20
   The audit path for d0 is [mth(1,2), mth(2,4), mth(4,7)].
   The audit path for d3 is [mth(2,3), mth(0,2), mth(4,7)].
   The audit path for d4 is [mth(5,6), mth(6,7), mth(0,4)].
   The audit path for d6 is [mth(4,6), mth(0,4)].



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Subject: [therightkey] Updated I-D available
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https://datatracker.ietf.org/doc/draft-laurie-pki-sunlight/?include_text=1

From paul@marvell.com  Thu Nov 29 07:55:12 2012
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From: Paul Lambert <paul@marvell.com>
To: "therightkey@ietf.org" <therightkey@ietf.org>, Ben Laurie <benl@google.com>
Date: Thu, 29 Nov 2012 07:55:08 -0800
Thread-Topic: Another suggested change
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>Structure of the Merkle audit proof:
>
>       struct {
>           opaque sha256_hash[32];
>       } MerkleNode;
>
>       struct {
>           Version version;
>           LogID id;
>           uint64 tree_size;
>           uint64 timestamp;   <------------------------------ not
>necessary
>           uint64 leaf_index;
>           MerkleNode audit_path<0..2^16-1>;
>           TreeHeadSignature tree_head_signature;  <--- contains timestamp
>       } MerkleAuditProof;
>
>


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Cc: "therightkey@ietf.org" <therightkey@ietf.org>
Subject: Re: [therightkey] Another suggested change
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On 29 November 2012 15:55, Paul Lambert <paul@marvell.com> wrote:
>
>
>
>>Structure of the Merkle audit proof:
>>
>>       struct {
>>           opaque sha256_hash[32];
>>       } MerkleNode;
>>
>>       struct {
>>           Version version;
>>           LogID id;
>>           uint64 tree_size;
>>           uint64 timestamp;   <------------------------------ not
>>necessary
>>           uint64 leaf_index;
>>           MerkleNode audit_path<0..2^16-1>;
>>           TreeHeadSignature tree_head_signature;  <--- contains timestamp
>>       } MerkleAuditProof;

Not sure why you think the timestamp is not needed?

>>
>>
>

From ekasper@google.com  Fri Nov 30 06:28:32 2012
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References: <D57AB653-9738-45D4-8E66-38C1981F801B@nymbus.net> <CCDCC4DD.78C0%paul@marvell.com> <CABrd9SRy7z191SAspvV9QmL7+enhAA7c86v+h78mtT1V=KDvXg@mail.gmail.com>
Date: Fri, 30 Nov 2012 15:28:30 +0100
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From: Emilia Kasper <ekasper@google.com>
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Cc: Paul Lambert <paul@marvell.com>, "therightkey@ietf.org" <therightkey@ietf.org>
Subject: Re: [therightkey] Another suggested change
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On Fri, Nov 30, 2012 at 3:17 PM, Ben Laurie <benl@google.com> wrote:
> On 29 November 2012 15:55, Paul Lambert <paul@marvell.com> wrote:
>>
>>
>>
>>>Structure of the Merkle audit proof:
>>>
>>>       struct {
>>>           opaque sha256_hash[32];
>>>       } MerkleNode;
>>>
>>>       struct {
>>>           Version version;
>>>           LogID id;
>>>           uint64 tree_size;
>>>           uint64 timestamp;   <------------------------------ not
>>>necessary
>>>           uint64 leaf_index;
>>>           MerkleNode audit_path<0..2^16-1>;
>>>           TreeHeadSignature tree_head_signature;  <--- contains timestamp
>>>       } MerkleAuditProof;
>
> Not sure why you think the timestamp is not needed?

I'm glad to see people verifying the sanity of the structures!

I think I know where the confusion is - in TLS notation,
digitally-signed struct  { } is a signature on the data in the struct;
it does not include the data itself. So TreeHeadSignature is a
signature over timestamp and other bits, but you need to include all
bits needed for verification separately.

>>>
>>>
>>
> _______________________________________________
> therightkey mailing list
> therightkey@ietf.org
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From paul@marvell.com  Fri Nov 30 09:27:41 2012
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From: Paul Lambert <paul@marvell.com>
To: Ben Laurie <benl@google.com>
Date: Fri, 30 Nov 2012 09:27:35 -0800
Thread-Topic: Another suggested change
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Cc: "therightkey@ietf.org" <therightkey@ietf.org>
Subject: Re: [therightkey] Another suggested change
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On 11/30/12 6:17 AM, "Ben Laurie" <benl@google.com> wrote:

>On 29 November 2012 15:55, Paul Lambert <paul@marvell.com> wrote:
>>
>>
>>
>>>Structure of the Merkle audit proof:
>>>
>>>       struct {
>>>           opaque sha256_hash[32];
>>>       } MerkleNode;
>>>
>>>       struct {
>>>           Version version;
>>>           LogID id;
>>>           uint64 tree_size;
>>>           uint64 timestamp;   <------------------------------ not
>>>necessary
>>>           uint64 leaf_index;
>>>           MerkleNode audit_path<0..2^16-1>;
>>>           TreeHeadSignature tree_head_signature;  <--- contains
>>>timestamp
>>>       } MerkleAuditProof;
>
>Not sure why you think the timestamp is not needed?

There are two timestamps =8A  one in the tree_head_signature and one on the
Audit Proof. =20
The timestamp within tree_head_signature is very useful.
Not sure the intent of the usage and benefit of the additional timestamp
on MerkleAuditProof.
Seems that the timestamp with the tree_head_signature would always be the
definitive creation time.

However =8A 03 no longer has the MerkelAuditProof structure


The SignedCertificateTimestamp is similar and has two timestamps. Clarity
on the need and utilization of two time values would be useful.


Paul
>
>>>
>>>
>>


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From: Paul Lambert <paul@marvell.com>
To: Emilia Kasper <ekasper@google.com>, Ben Laurie <benl@google.com>
Date: Fri, 30 Nov 2012 17:39:29 -0800
Thread-Topic: [therightkey] Another suggested change
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On 11/30/12 6:28 AM, "Emilia Kasper" <ekasper@google.com> wrote:

>On Fri, Nov 30, 2012 at 3:17 PM, Ben Laurie <benl@google.com> wrote:
>> On 29 November 2012 15:55, Paul Lambert <paul@marvell.com> wrote:
>>>
>>>
>>>
>>>>Structure of the Merkle audit proof:
>>>>
>>>>       struct {
>>>>           opaque sha256_hash[32];
>>>>       } MerkleNode;
>>>>
>>>>       struct {
>>>>           Version version;
>>>>           LogID id;
>>>>           uint64 tree_size;
>>>>           uint64 timestamp;   <------------------------------ not
>>>>necessary
>>>>           uint64 leaf_index;
>>>>           MerkleNode audit_path<0..2^16-1>;
>>>>           TreeHeadSignature tree_head_signature;  <--- contains
>>>>timestamp
>>>>       } MerkleAuditProof;
>>
>> Not sure why you think the timestamp is not needed?
>
>I'm glad to see people verifying the sanity of the structures!
>
>I think I know where the confusion is - in TLS notation,
>digitally-signed struct  { } is a signature on the data in the struct;
>it does not include the data itself. So TreeHeadSignature is a
>signature over timestamp and other bits, but you need to include all
>bits needed for verification separately.

Thanks! Yes, I was confused by the struct usage as a definition of "input"
to the signature =8A just need to read the text an not just the code :-)


Paul

PS - seems like we should have better ways to define protocols =8A
PPS - still don't see that the audit path algorithm is correct, should be:

k =3D k1 + largestPower2(k2-k1)


  PATH(m, D[n]) =3D PATH(m, D[k1:k]) : MTH(D[k:k2]) for m < k; and

  PATH(m, D[n]) =3D PATH(m, D[k:k2]) : MTH(D[k1:k]) for m >=3D k,




>
>>>>
>>>>
>>>
>> _______________________________________________
>> therightkey mailing list
>> therightkey@ietf.org
>> https://www.ietf.org/mailman/listinfo/therightkey

