
From nico@cryptonector.com  Fri May  3 12:39:46 2013
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From: Nico Williams <nico@cryptonector.com>
To: Peter Saint-Andre <stpeter@stpeter.im>, precis@ietf.org, kitten@ietf.org,  Alexey Melnikov <alexey.melnikov@isode.com>
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Subject: Re: [kitten] Fwd: I-D Action: draft-ietf-precis-saslprepbis-01.txt
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Please forgive my apparent apathy.  I lost track of this due to business travel.

I'm not sure where the case mapping requirement for usernames came
from.  I guess it has something to do with the Turkish I and such.  I
can't say I'm excited about this case mapping requirement; if anything
it strikes as silly.

Why would we apply mappings to usernames (which are sent on the wire)
that we don't apply to passwords (which servers generally don't get
the plaintext of)?  We need mappings for passwords to make password
entry reliable.  The same does NOT apply to usernames.

Also, looking at SASLprep and PRECIS, I see no mention of query
strings vs. display vs. storage.  These distinctions matter.  But
maybe I'm just failing to search for the right terms.  Heck, we're not
even told whether these rules should be applied by the client, the
server, or both.

Anyways, I'm for applying as few transformations as possible to
usernames on the *client* side and leaving the server to apply
RECOMMENDED, and a few REQUIRED rules for matching.  I don't see room
for case folding in general, but I do for specific cases (e.g.,
Turkish I handling).

If this review is too late to make a difference, well, c'est la vie.
But do give the above some thought before rejecting my comments for
being late.  Once more, I'm sorry I let this slip.

Nico
--

From shawn.emery@oracle.com  Fri May  3 23:02:22 2013
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Subject: [kitten] kitten WG Interim Meeting Information
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Topic: KITTEN WG Interim
Date: Monday, May 6, 2013
Time: 8:00 am, Pacific Daylight Time (San Francisco, GMT-07:00)
Meeting Number: 640 049 742
Meeting Password: 1234


-------------------------------------------------------
To join the online meeting (Now from mobile devices!)
-------------------------------------------------------
1. Go to 
https://ietf.webex.com/ietf/j.php?ED=179545787&UID=1381218722&PW=NYTQ2YTA5MjY4&RT=MiM0 

2. If requested, enter your name and email address.
3. If a password is required, enter the meeting password: 1234
4. Click "Join".

To view in other time zones or languages, please click the link:
https://ietf.webex.com/ietf/j.php?ED=179545787&UID=1381218722&PW=NYTQ2YTA5MjY4&ORT=MiM0 


-------------------------------------------------------
To join the audio conference only
-------------------------------------------------------
Call-in toll number (US/Canada): 1-650-479-3208

Access code:640 049 742

The IETF WebEx has a "use computer for audio" feature that allows a user
to participate using their computer and a headset.  However, the quality
of the audio tends to be quite variable, and those who use this feature
should mute themselves via the WebEx interface when not speaking to
avoid causing echo.

Users can also access the call-in number via Skype:

1.  Bring up your Skype application.
2.  Bring up your browser, and go to the WebEx URL.
3.  Enter your name and email address.
4.  Close the WebEx window prompting for a phone number.
5.  Select the "info" tab at the top of the WebEx browser page.
6.  Go to Skype, and dial the U.S. number from the meeting
     announcement.
7.  Click on the DialPad tab on the Skype window.
8.  Use the virtual keypad to enter the meeting number followed by #.
9.  Use the virtual keypad to enter your attendee ID followed by #.

-------------------------------------------------------
For assistance
-------------------------------------------------------
1. Go to https://ietf.webex.com/ietf/mc
2. On the left navigation bar, click "Support".

You can contact me at:
cmorgan@amsl.com <mailto:cmorgan@amsl.com>
1-510-492-4085

To add this meeting to your calendar program (for example Microsoft 
Outlook), click this link:
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The playback of UCF (Universal Communications Format) rich media files 
requires appropriate players. To view this type of rich media files in 
the meeting, please check whether you have the players installed on your 
computer by going to https://ietf.webex.com/ietf/systemdiagnosis.php.

Sign up for a free trial of WebEx
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CCP:+16504793208x640049742#

IMPORTANT NOTICE: This WebEx service includes a feature that allows 
audio and any documents and other materials exchanged or viewed during 
the session to be recorded. By joining this session, you automatically 
consent to such recordings. If you do not consent to the recording, 
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    <div class="moz-forward-container"><font face="Tahoma, Arial,
        sans-serif, Helvetica, Geneva" size="2"> Topic: KITTEN WG
        Interim <br>
        Date: Monday, May 6, 2013 <br>
        Time: 8:00 am, Pacific Daylight Time (San Francisco, GMT-07:00)
        <br>
        Meeting Number: 640 049 742 <br>
        Meeting Password: 1234 <br>
        <br>
        <br>
        ------------------------------------------------------- <br>
        To join the online meeting (Now from mobile devices!) <br>
        ------------------------------------------------------- <br>
        1. Go to <a moz-do-not-send="true"
href="https://ietf.webex.com/ietf/j.php?ED=179545787&amp;UID=1381218722&amp;PW=NYTQ2YTA5MjY4&amp;RT=MiM0"
          target="_blank">https://ietf.webex.com/ietf/j.php?ED=179545787&amp;UID=1381218722&amp;PW=NYTQ2YTA5MjY4&amp;RT=MiM0</a>
        <br>
        2. If requested, enter your name and email address. <br>
        3. If a password is required, enter the meeting password: 1234 <br>
        4. Click "Join". <br>
        <br>
        To view in other time zones or languages, please click the link:
        <br>
        <a moz-do-not-send="true"
href="https://ietf.webex.com/ietf/j.php?ED=179545787&amp;UID=1381218722&amp;PW=NYTQ2YTA5MjY4&amp;ORT=MiM0"
          target="_blank">https://ietf.webex.com/ietf/j.php?ED=179545787&amp;UID=1381218722&amp;PW=NYTQ2YTA5MjY4&amp;ORT=MiM0</a>
        <br>
        <br>
        ------------------------------------------------------- <br>
        To join the audio conference only <br>
        ------------------------------------------------------- <br>
        Call-in toll number (US/Canada): 1-650-479-3208 <br>
        <br>
        Access code:640 049 742</font><font face="Tahoma, Arial,
        sans-serif, Helvetica, Geneva" size="2"><font size="2"><font
            size="2"><font size="2"><font size="2"><font size="2"><font
                    size="2"><font size="2"></font><br>
                  </font></font></font></font></font></font></font>
      <pre wrap="">The IETF WebEx has a "use computer for audio" feature that allows a user
to participate using their computer and a headset.  However, the quality
of the audio tends to be quite variable, and those who use this feature
should mute themselves via the WebEx interface when not speaking to
avoid causing echo.

Users can also access the call-in number via Skype:

1.  Bring up your Skype application.
2.  Bring up your browser, and go to the WebEx URL.
3.  Enter your name and email address.
4.  Close the WebEx window prompting for a phone number.
5.  Select the "info" tab at the top of the WebEx browser page.
6.  Go to Skype, and dial the U.S. number from the meeting 
    announcement.
7.  Click on the DialPad tab on the Skype window.
8.  Use the virtual keypad to enter the meeting number followed by #.
9.  Use the virtual keypad to enter your attendee ID followed by #.</pre>
      <font face="Tahoma, Arial, sans-serif, Helvetica, Geneva" size="2">
        ------------------------------------------------------- <br>
        For assistance <br>
        ------------------------------------------------------- <br>
        1. Go to <a moz-do-not-send="true"
          href="https://ietf.webex.com/ietf/mc" target="_blank">https://ietf.webex.com/ietf/mc</a>
        <br>
        2. On the left navigation bar, click "Support". <br>
        <br>
        You can contact me at: <br>
        <a moz-do-not-send="true" href="mailto:cmorgan@amsl.com">cmorgan@amsl.com</a>
        <br>
        1-510-492-4085 <br>
        <br>
        To add this meeting to your calendar program (for example
        Microsoft Outlook), click this link: <br>
        <a moz-do-not-send="true"
href="https://ietf.webex.com/ietf/j.php?ED=179545787&amp;UID=1381218722&amp;ICS=MI&amp;LD=1&amp;RD=2&amp;ST=1&amp;SHA2=AAAAAqaLd3iTjOQdFMoQ4QudQhNdYxPyqtufO60he9MbQwkT&amp;RT=MiM0"
          target="_blank">https://ietf.webex.com/ietf/j.php?ED=179545787&amp;UID=1381218722&amp;ICS=MI&amp;LD=1&amp;RD=2&amp;ST=1&amp;SHA2=AAAAAqaLd3iTjOQdFMoQ4QudQhNdYxPyqtufO60he9MbQwkT&amp;RT=MiM0</a>
        <br>
        <br>
        The playback of UCF (Universal Communications Format) rich media
        files requires appropriate players. To view this type of rich
        media files in the meeting, please check whether you have the
        players installed on your computer by going to <a
          moz-do-not-send="true"
          href="https://ietf.webex.com/ietf/systemdiagnosis.php">https://ietf.webex.com/ietf/systemdiagnosis.php</a>.
        <br>
        <br>
        Sign up for a free trial of WebEx <br>
        <a moz-do-not-send="true"
          href="http://www.webex.com/go/mcemfreetrial" target="_blank">http://www.webex.com/go/mcemfreetrial</a>
        <br>
        <br>
        <a moz-do-not-send="true" href="http://www.webex.com"
          target="_blank">http://www.webex.com</a> <br>
        <br>
        CCP:+16504793208x640049742# <br>
        <br>
        IMPORTANT NOTICE: This WebEx service includes a feature that
        allows audio and any documents and other materials exchanged or
        viewed during the session to be recorded. By joining this
        session, you automatically consent to such recordings. If you do
        not consent to the recording, discuss your concerns with the
        meeting host prior to the start of the recording or do not join
        the session. Please note that any such recordings may be subject
        to discovery in the event of litigation.<br>
        <br>
      </font></div>
  </body>
</html>

--------------060305040005040003090209--

From kaduk@mit.edu  Sun May  5 13:24:29 2013
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Cc: kitten@ietf.org
Subject: Re: [kitten] -02 of GSS_C_CHANNEL_BOUND_FLAG I-D submitted
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On Fri, 22 Feb 2013, Nico Williams wrote:

> Version -02, using the "empty sec context constructor" design has been
> submitted.
>
> http://www.ietf.org/id/draft-williams-kitten-channel-bound-flag-02.txt
> http://tools.ietf.org/html/draft-williams-kitten-channel-bound-flag-02
> http://tools.ietf.org/rfcdiff?difftype=--hwdiff&url2=draft-williams-kitten-channel-bound-flag-02.txt
>
> (Hmm, I just realized that we should say what happens when
> GSS_Delete_sec_context() is called on an empty sec context handle,
> namely that no deletion context token is to be generated.)

(Yes, you should.)

It looks like I never commented on the channel bound flag on-list.
The concept of the -02 draft, with empty security context handles, does 
seem more appealing than the -00's flags on credential handles.

In 2.1, a NULL context is usually spelled GSS_C_NO_CONTEXT, and it might 
be good to explicitly call out that this document is changing the expected 
behavior of GSS_{Init,Accept}_sec_context() (as opposed to doing so in 
passing).

In 2.2.1, I assume that the use of 64-bit types for the flags arguments 
(as opposed to the 32-bit types in the C bindings for 
gss_init_sec_context()) is an intentional attempt to increase the number 
of flags available?

In section 3, the fourth bullet point (applications using the 
channel_bound flag) does not specify the behavior when both peers provide 
bindings but the bindings differ.  This case is covered by the first 
bullet point, but a reminder might help the reader.

-Ben

From kaduk@mit.edu  Sun May  5 14:53:39 2013
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Date: Sun, 5 May 2013 17:53:28 -0400 (EDT)
From: Benjamin Kaduk <kaduk@MIT.EDU>
To: kitten@ietf.org
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Subject: Re: [kitten] I-D Action: draft-ietf-kitten-iakerb-00.txt
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On Wed, 10 Apr 2013, internet-drafts@ietf.org wrote:

>
> A New Internet-Draft is available from the on-line Internet-Drafts directories.
> This draft is a work item of the Common Authentication Technology Next Generation Working Group of the IETF.
>
> 	Title           : Initial and Pass Through Authentication Using Kerberos V5 and the GSS- API (IAKERB)
> 	Author(s)       : Jim Schaad
>                          Larry Zhu
>                          Jeffery Altman
> 	Filename        : draft-ietf-kitten-iakerb-00.txt
> 	Pages           : 9
> 	Date            : 2013-04-10
>
> Abstract:
>   This document defines extensions to the Kerberos protocol and the
>   GSS-API Kerberos mechanism that enable a GSS-API Kerberos client to
>   exchange messages with the KDC using the GSS-API acceptor as the

I think the last "the" on this line should be "a".

Likewise for where "the proxy" appears in the introduction's last 
paragraph.

>   proxy, by encapsulating the Kerberos messages inside GSS-API tokens.
>   With these extensions a client can obtain Kerberos tickets for
>   services where the KDC is not accessible to the client, but is
>   accessible to the application server.

Other comments:


Also in the introduction, no expansion or motivation for the name/term 
"IAKERB" is given when it is first introduced.  (None is given elsewhere 
in the document that I can see, either.)

The top of page 4 seems to have some editing errors, referring to a 
"GSS-API server" (not acceptor), and then in the following paragraph does 
not specify that the KRB_ERROR message should be used in the IAKERB_PROXY 
message in place of an actual KDC reply.

Hmm, "GSS-API server" appears in at least one other place as well.

In the security considerations, the sentence "To reduce attack surface, 
firewall filters can be applied to allow from which hosts the client 
requests can be proxied and the proxy can further restrict the set of 
realms to which the requests can be proxied." has an unusual, perhaps even 
incorrect, sentence structure (in particular "allow from which hosts").

I think it would be feasible to extract the necessary bits from PKU2U and 
include them in this document, but defer to tomorrow's discussion.

-Ben

From kaduk@mit.edu  Sun May  5 15:02:57 2013
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Date: Sun, 5 May 2013 18:02:47 -0400 (EDT)
From: Benjamin Kaduk <kaduk@MIT.EDU>
To: Nico Williams <nico@cryptonector.com>
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Subject: Re: [kitten] Simplified and async API
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On Fri, 22 Feb 2013, Nico Williams wrote:

> Too late for submitting -00s.  So here:
>
> https://raw.github.com/nicowilliams/kitten/master/gss-step-ctx.txt

Did this ever get submitted as an I-D?  I don't see it on the 
datatracker...

-Ben

From internet-drafts@ietf.org  Sun May  5 15:35:03 2013
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Subject: [kitten] I-D Action: draft-ietf-kitten-sasl-saml-ec-08.txt
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A New Internet-Draft is available from the on-line Internet-Drafts director=
ies.
 This draft is a work item of the Common Authentication Technology Next Gen=
eration Working Group of the IETF.

	Title           : SAML Enhanced Client SASL and GSS-API Mechanisms
	Author(s)       : Scott Cantor
                          Simon Josefsson
	Filename        : draft-ietf-kitten-sasl-saml-ec-08.txt
	Pages           : 32
	Date            : 2013-05-05

Abstract:
   Security Assertion Markup Language (SAML) 2.0 is a generalized
   framework for the exchange of security-related information between
   asserting and relying parties.  Simple Authentication and Security
   Layer (SASL) and the Generic Security Service Application Program
   Interface (GSS-API) are application frameworks to facilitate an
   extensible authentication model.  This document specifies a SASL and
   GSS-API mechanism for SAML 2.0 that leverages the capabilities of a
   SAML-aware "enhanced client" to address significant barriers to
   federated authentication in a manner that encourages reuse of
   existing SAML bindings and profiles designed for non-browser
   scenarios.


The IETF datatracker status page for this draft is:
https://datatracker.ietf.org/doc/draft-ietf-kitten-sasl-saml-ec

There's also a htmlized version available at:
http://tools.ietf.org/html/draft-ietf-kitten-sasl-saml-ec-08

A diff from the previous version is available at:
http://www.ietf.org/rfcdiff?url2=3Ddraft-ietf-kitten-sasl-saml-ec-08


Internet-Drafts are also available by anonymous FTP at:
ftp://ftp.ietf.org/internet-drafts/


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Subject: Re: [kitten] New Version Notification for	draft-ietf-kitten-iakerb-00.txt
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Today I did a more careful comparison of draft-zhu-ws-kerb vs.
draft-ietf-kitten-iakerb, and uncovered a second superficial difference.
 draft-zhu-ws-kerb states:

   The initial context establishment token of IAKERB MUST have the
   generic token framing described in section 3.1 of [RFC2743] with the
   mechanism OID being id-kerberos-iakerb, and any subsequent IAKERB
   context establishment token MUST NOT have this token framing.

while draft-kitten-ietf-iakerb states:

   All context establishment token of IAKERB MUST have the generic token
   framing described in section 3.1 of [RFC2743] with the mechanism OID
   being id-kerberos-iakerb.

Luckily, MIT's implementation allows framing to be present for all
context establishment tokens.  This makes the situation tractable; we
can change our code to always generate framing, without breaking
compatibility with ourselves.

I will send a separate message (in a different thread) with a list of
options for handling the compatibility differences.


From ghudson@mit.edu  Mon May  6 11:34:37 2013
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From: Greg Hudson <ghudson@MIT.EDU>
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Subject: [kitten] Options for IAKERB compatibility issue
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Here are some options for addressing the superficial incompatibilities
between MIT's implementation of draft-zhu-ws-kerb and the current
draft-kitten-ietf-iakerb (see [1] and [2] for details).

1. We can ignore the problem.  MIT's implementation won't be compatible
   with the standard and we won't be able to make it compatible without
   breaking compatibility with ourselves.

2. We can revert to the draft-zhu-ws-kerb superficialities.  This works
   great for MIT, but presents OSX with the same problem as MIT would
   have in #1.

3. We can make the standard semi-compatible with both implementations:
   - always generate generic token framing
   - process framed or unframed messages after the first initiator token
   - acceptors must process either kind of finished extension
   - initiators may send either kind of finished extension
   A standard acceptor would work with MIT and OSX initiators.  A
   standard initiator can only be compatible with MIT or OSX acceptors
   (it has to guess which type of finished extension to send), but will
   always be compatible with a standard acceptor.

4. Possibly in addition to #3, we could extend IAKERB-HEADER with a new
   field that acts as an "I implement the standard" cue.  This option
   would give MIT a path to generating the pku2u-style of finished
   extension, but it doesn't create a better compatibility matrix than
   just requiring acceptors to allow both kinds of finished extension.

5. We can define a new mech OID for the standard.  I don't like this
   option because I don't like proliferating krb5 mech OIDs.  It also
   means the standard wouldn't interoperate with either OSX's or Apple's
   implementation.

[1] http://www.ietf.org/mail-archive/web/kitten/current/msg03919.html
[2] http://www.ietf.org/mail-archive/web/kitten/current/msg03984.html

From nico@cryptonector.com  Mon May  6 11:56:51 2013
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Subject: Re: [kitten] Options for IAKERB compatibility issue
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On Mon, May 6, 2013 at 1:34 PM, Greg Hudson <ghudson@mit.edu> wrote:
> 5. We can define a new mech OID for the standard.  I don't like this
>    option because I don't like proliferating krb5 mech OIDs.  It also
>    means the standard wouldn't interoperate with either OSX's or Apple's
>    implementation.

The new mech OID would interop with one of the existing
implementations, and the other implementation would have to support
the old and new mech OIDs in order to get past non-iteroperability.
What's wrong with that?

In any case, something has to be done, some tears may have to be shed.
 It'd be useful to have an idea of what deployments exist.  Perhaps we
should start by polling for deployments.

Nico
--

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Subject: Re: [kitten] Options for IAKERB compatibility issue
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On 05/06/2013 02:56 PM, Nico Williams wrote:
> On Mon, May 6, 2013 at 1:34 PM, Greg Hudson <ghudson@mit.edu> wrote:
>> 5. We can define a new mech OID for the standard.  I don't like this
>>    option because I don't like proliferating krb5 mech OIDs.  It also
>>    means the standard wouldn't interoperate with either OSX's or Apple's
>>    implementation.

> The new mech OID would interop with one of the existing
> implementations

Not under any reasonable definition of "interoperate".  If the standard
uses a different OID from 1.3.6.1.5.2.5, then an implementation of the
standard won't interoperate with an existing MIT krb5 or OSX implementation.

One could potentially use the same or similar code for both OIDs, but
that's not interoperating; that's code sharing.


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To: Greg Hudson <ghudson@MIT.EDU>
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Subject: Re: [kitten] Options for IAKERB compatibility issue
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2 is not an option, its 5 or 1. prefer 1. doubtless after doing interop =
testing we'll find more issues.

Love


6 maj 2013 kl. 11:34 skrev Greg Hudson <ghudson@MIT.EDU>:

> Here are some options for addressing the superficial incompatibilities
> between MIT's implementation of draft-zhu-ws-kerb and the current
> draft-kitten-ietf-iakerb (see [1] and [2] for details).
>=20
> 1. We can ignore the problem.  MIT's implementation won't be =
compatible
>   with the standard and we won't be able to make it compatible without
>   breaking compatibility with ourselves.
>=20
> 2. We can revert to the draft-zhu-ws-kerb superficialities.  This =
works
>   great for MIT, but presents OSX with the same problem as MIT would
>   have in #1.
>=20
> 3. We can make the standard semi-compatible with both implementations:
>   - always generate generic token framing
>   - process framed or unframed messages after the first initiator =
token
>   - acceptors must process either kind of finished extension
>   - initiators may send either kind of finished extension
>   A standard acceptor would work with MIT and OSX initiators.  A
>   standard initiator can only be compatible with MIT or OSX acceptors
>   (it has to guess which type of finished extension to send), but will
>   always be compatible with a standard acceptor.
>=20
> 4. Possibly in addition to #3, we could extend IAKERB-HEADER with a =
new
>   field that acts as an "I implement the standard" cue.  This option
>   would give MIT a path to generating the pku2u-style of finished
>   extension, but it doesn't create a better compatibility matrix than
>   just requiring acceptors to allow both kinds of finished extension.
>=20
> 5. We can define a new mech OID for the standard.  I don't like this
>   option because I don't like proliferating krb5 mech OIDs.  It also
>   means the standard wouldn't interoperate with either OSX's or =
Apple's
>   implementation.
>=20
> [1] http://www.ietf.org/mail-archive/web/kitten/current/msg03919.html
> [2] http://www.ietf.org/mail-archive/web/kitten/current/msg03984.html
> _______________________________________________
> Kitten mailing list
> Kitten@ietf.org
> https://www.ietf.org/mailman/listinfo/kitten


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<html><head><meta http-equiv=3D"Content-Type" content=3D"text/html =
charset=3Dus-ascii"></head><body style=3D"word-wrap: break-word; =
-webkit-nbsp-mode: space; -webkit-line-break: =
after-white-space;"><div><br></div><div>2 is not an option, its 5 or 1. =
prefer 1. doubtless after doing interop testing we'll find more =
issues.</div><div><br></div><div>Love</div><div><br></div><br><div><div>6 =
maj 2013 kl. 11:34 skrev Greg Hudson &lt;<a =
href=3D"mailto:ghudson@MIT.EDU">ghudson@MIT.EDU</a>&gt;:</div><br =
class=3D"Apple-interchange-newline"><blockquote type=3D"cite"><div =
style=3D"letter-spacing: normal; orphans: auto; text-align: start; =
text-indent: 0px; text-transform: none; white-space: normal; widows: =
auto; word-spacing: 0px; -webkit-text-stroke-width: 0px;">Here are some =
options for addressing the superficial incompatibilities<br>between =
MIT's implementation of draft-zhu-ws-kerb and the =
current<br>draft-kitten-ietf-iakerb (see [1] and [2] for =
details).<br><br>1. We can ignore the problem. &nbsp;MIT's =
implementation won't be compatible<br>&nbsp;&nbsp;with the standard and =
we won't be able to make it compatible without<br>&nbsp;&nbsp;breaking =
compatibility with ourselves.<br><br>2. We can revert to the =
draft-zhu-ws-kerb superficialities. &nbsp;This =
works<br>&nbsp;&nbsp;great for MIT, but presents OSX with the same =
problem as MIT would<br>&nbsp;&nbsp;have in #1.<br><br>3. We can make =
the standard semi-compatible with both implementations:<br>&nbsp;&nbsp;- =
always generate generic token framing<br>&nbsp;&nbsp;- process framed or =
unframed messages after the first initiator token<br>&nbsp;&nbsp;- =
acceptors must process either kind of finished =
extension<br>&nbsp;&nbsp;- initiators may send either kind of finished =
extension<br>&nbsp;&nbsp;A standard acceptor would work with MIT and OSX =
initiators. &nbsp;A<br>&nbsp;&nbsp;standard initiator can only be =
compatible with MIT or OSX acceptors<br>&nbsp;&nbsp;(it has to guess =
which type of finished extension to send), but =
will<br>&nbsp;&nbsp;always be compatible with a standard =
acceptor.<br><br>4. Possibly in addition to #3, we could extend =
IAKERB-HEADER with a new<br>&nbsp;&nbsp;field that acts as an "I =
implement the standard" cue. &nbsp;This option<br>&nbsp;&nbsp;would give =
MIT a path to generating the pku2u-style of =
finished<br>&nbsp;&nbsp;extension, but it doesn't create a better =
compatibility matrix than<br>&nbsp;&nbsp;just requiring acceptors to =
allow both kinds of finished extension.<br><br>5. We can define a new =
mech OID for the standard. &nbsp;I don't like this<br>&nbsp;&nbsp;option =
because I don't like proliferating krb5 mech OIDs. &nbsp;It =
also<br>&nbsp;&nbsp;means the standard wouldn't interoperate with either =
OSX's or Apple's<br>&nbsp;&nbsp;implementation.<br><br>[1]<span =
class=3D"Apple-converted-space">&nbsp;</span><a =
href=3D"http://www.ietf.org/mail-archive/web/kitten/current/msg03919.html"=
>http://www.ietf.org/mail-archive/web/kitten/current/msg03919.html</a><br>=
[2]<span class=3D"Apple-converted-space">&nbsp;</span><a =
href=3D"http://www.ietf.org/mail-archive/web/kitten/current/msg03984.html"=
>http://www.ietf.org/mail-archive/web/kitten/current/msg03984.html</a><br>=
_______________________________________________<br>Kitten mailing =
list<br><a href=3D"mailto:Kitten@ietf.org">Kitten@ietf.org</a><br><a =
href=3D"https://www.ietf.org/mailman/listinfo/kitten">https://www.ietf.org=
/mailman/listinfo/kitten</a></div></blockquote></div><br></body></html>=

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Subject: Re: [kitten] Options for IAKERB compatibility issue
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On 05/07/2013 02:02 PM, Love Hörnquist Åstrand wrote:
> 2 is not an option, its 5 or 1. prefer 1. doubtless after doing interop
> testing we'll find more issues.

Can you please explain your objection to #3?



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7 maj 2013 kl. 11:16 skrev Greg Hudson <ghudson@MIT.EDU>:

> On 05/07/2013 02:02 PM, Love H=F6rnquist =C5strand wrote:
>> 2 is not an option, its 5 or 1. prefer 1. doubtless after doing =
interop
>> testing we'll find more issues.
>=20
> Can you please explain your objection to #3?

it require changes. I fine with saying REQUIRE framing, but if you want =
to interop, you better consider accept unframed too.

Love


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<html><head><meta http-equiv=3D"Content-Type" content=3D"text/html =
charset=3Diso-8859-1"></head><body style=3D"word-wrap: break-word; =
-webkit-nbsp-mode: space; -webkit-line-break: =
after-white-space;"><br><div><div>7 maj 2013 kl. 11:16 skrev Greg Hudson =
&lt;<a href=3D"mailto:ghudson@MIT.EDU">ghudson@MIT.EDU</a>&gt;:</div><br =
class=3D"Apple-interchange-newline"><blockquote type=3D"cite"><div =
style=3D"letter-spacing: normal; orphans: auto; text-align: start; =
text-indent: 0px; text-transform: none; white-space: normal; widows: =
auto; word-spacing: 0px; -webkit-text-stroke-width: 0px;">On 05/07/2013 =
02:02 PM, Love H=F6rnquist =C5strand wrote:<br><blockquote type=3D"cite">2=
 is not an option, its 5 or 1. prefer 1. doubtless after doing =
interop<br>testing we'll find more issues.<br></blockquote><br>Can you =
please explain your objection to #3?</div></blockquote></div><br><div>it =
require changes. I fine with saying REQUIRE framing, but if you want to =
interop, you better consider accept unframed =
too.</div><div><br></div><div>Love</div><div><br></div></body></html>=

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Date: Tue, 07 May 2013 14:38:28 -0400
From: Greg Hudson <ghudson@MIT.EDU>
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Subject: Re: [kitten] Options for IAKERB compatibility issue
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I just realized that we can use the absence of framing to detect an MIT
IAKERB implementation.  This makes the problem much more tractable.

So here is option 6 (a variation of option 1), which is my preferred option:

6. The main text of the standard stays as-is.  We add an appendix
describing how to be compatible with the current MIT implementation:

- Process messages without framing after the first initiator token.

- If you're the initiator and you see an unframed acceptor token, use
the MIT variant of the finished extension in the AP-REQ  checksum
(extension type 1 and key usage 42).

- If you're the acceptor, process either variant of the finished extension.

If we go in this direction, the MIT implementation can change to
generate framing on all tokens, send the standard variant of the
finished extension in the AP-REQ checksum if it sees a framed acceptor
token, and process either variant of the finished extension in the acceptor.

Sorry I didn't realize this yesterday; I could have cut out a
substantial amount of noise.


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Subject: Re: [kitten] Options for IAKERB compatibility issue
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Greg, presumably MIt would need to send unframed messages if it gets an
unframed acceptor message as well.

That is, I think your option works but your description of the appendix
is incomplete.

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Cc: kitten@ietf.org
Subject: Re: [kitten] Options for IAKERB compatibility issue
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On 05/08/2013 11:47 AM, Sam Hartman wrote:
> Greg, presumably MIt would need to send unframed messages if it gets an
> unframed acceptor message as well.

No, this is unnecessary.  Our implementation will happily process framed
messages for all context tokens.  (Verified experimentally.)


From hartmans@mit.edu  Fri May 10 09:45:16 2013
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Subject: [kitten] Berlin Meeting: Agenda Items and Attendance
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Hi.

the chairs would like to gage how much time we'll need in Berlin.
We're wondering who will be able to attend and what agenda topics people
would like to cover.

Topics we expect to cover include:

1) GS2 updates (assuming principals are present)

2) Channel bound flag (assuming principals present)

3) Any updates to oauth, openid, saml and saml (again assuming we have
the right folks)

4) IANA documents

--Sam


From internet-drafts@ietf.org  Mon May 13 20:17:45 2013
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Subject: [kitten] I-D Action: draft-ietf-kitten-sasl-saml-ec-09.txt
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A New Internet-Draft is available from the on-line Internet-Drafts director=
ies.
 This draft is a work item of the Common Authentication Technology Next Gen=
eration Working Group of the IETF.

	Title           : SAML Enhanced Client SASL and GSS-API Mechanisms
	Author(s)       : Scott Cantor
                          Simon Josefsson
	Filename        : draft-ietf-kitten-sasl-saml-ec-09.txt
	Pages           : 38
	Date            : 2013-05-13

Abstract:
   Security Assertion Markup Language (SAML) 2.0 is a generalized
   framework for the exchange of security-related information between
   asserting and relying parties.  Simple Authentication and Security
   Layer (SASL) and the Generic Security Service Application Program
   Interface (GSS-API) are application frameworks to facilitate an
   extensible authentication model.  This document specifies a SASL and
   GSS-API mechanism for SAML 2.0 that leverages the capabilities of a
   SAML-aware "enhanced client" to address significant barriers to
   federated authentication in a manner that encourages reuse of
   existing SAML bindings and profiles designed for non-browser
   scenarios.


The IETF datatracker status page for this draft is:
https://datatracker.ietf.org/doc/draft-ietf-kitten-sasl-saml-ec

There's also a htmlized version available at:
http://tools.ietf.org/html/draft-ietf-kitten-sasl-saml-ec-09

A diff from the previous version is available at:
http://www.ietf.org/rfcdiff?url2=3Ddraft-ietf-kitten-sasl-saml-ec-09


Internet-Drafts are also available by anonymous FTP at:
ftp://ftp.ietf.org/internet-drafts/


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From: Sam Hartman <hartmans-ietf@mit.edu>
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Date: Tue, 14 May 2013 15:45:34 -0400
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Subject: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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Overall:

I think this is in fairly good shape. My comments seem to mostly fall
into two categories:

1) As chair I'm requesting that this document make no reference to
terminology or concepts introduced in the simplified profile in RFC
3961.
For the most part I'd expect this spec to refer only to RFC 3961
sections 3 and 4.

2) I recommend that the editors minimize references to RFC 3962; in
general repeating text from RFC 3962 is probably better than references.
This is a recommendation, not a requirement for progression; if the
editors consider the issue and believe that some references to RFC 3962
improve clarity or minimize the probability of specification or
implementation error, I'll be happy with that.


Detailed comments:



section 4:

The salt input to string_to_key is not under the control of a
specification of an RFC 3961 enctype.
It's inappropriate to place restrictions on the salt in this
specification.
Operationally what you may want is to encourage KDCs to include 128-bits
of randomness in the salt they use.
That doesn't belong as part of the encryption type specification; it may
be appropriate in the same document, clearly separated.

However, I think there are some issues related to keying services that
tend to come up if the salt contains random data. I know the MIT folks
explored this; I don't remember all the conclusions.

If this property is important, you'll almost certainly want to explore
advantages attackers could gain by causing a client to use the default
Kerberos salt--that is, just the principal and realm.  If we don't end
up liking the implications of that analysis we'll need to look at
changes broader in scope than are appropriate for an enctype
specification.


Section 5:


You seem to be using the function dr(), defined as part of the
simplified profile in RFC 3961, but your definition is different than
that in RFC 3961.  I find this notation confusing and would recommend
against adopting notation from the simplified profile.

Similarly, calling the key usage input to the key derivation n is
notation from the simplified profile, not from section 3 of RFC 3961 and
is highly confusing.


section 6:

The use of notation from the simplified profile is really problematic
here.

I think using cE, D and m is fine. I just think it would be desirable to
define them yourself rather than referencing the simplified profile
definitions.

I think I'd like to hear responses to these comments before deciding
whether we're ready for working group last call.

From ghudson@mit.edu  Tue May 14 16:00:37 2013
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Date: Tue, 14 May 2013 19:00:26 -0400
From: Greg Hudson <ghudson@MIT.EDU>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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I have an additional comment:

Section 6 notes that "[SP800-38A+] requires the plaintext length to be
greater than or equal to the block size" but gives no guidance on what
to do if the input is smaller than that.  This seems like a pretty
serious problem.

The RFC 3962 enctypes do not have this problem because they use a
confounder, which adds a block of input.  They did have to specify what
to do when the input length is 0, such that the cipher plaintext is
exactly one block.

From hartmans@mit.edu  Tue May 14 16:32:31 2013
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From: Sam Hartman <hartmans-ietf@mit.edu>
To: Greg Hudson <ghudson@MIT.EDU>
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>>>>> "Greg" == Greg Hudson <ghudson@MIT.EDU> writes:

    Greg> I have an additional comment: Section 6 notes that
    Greg> "[SP800-38A+] requires the plaintext length to be greater than
    Greg> or equal to the block size" but gives no guidance on what to
    Greg> do if the input is smaller than that.  This seems like a
    Greg> pretty serious problem.

    Greg> The RFC 3962 enctypes do not have this problem because they
    Greg> use a confounder, which adds a block of input.  They did have
    Greg> to specify what to do when the input length is 0, such that
    Greg> the cipher plaintext is exactly one block.

Thanks.  Yeah, I had missed this item because I was thinking there would
be a confounder, but that's not how the nonce is handled.

From shawn.emery@oracle.com  Wed May 15 00:28:40 2013
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Subject: [kitten] Consensus Calls
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The WG is making the following consensus calls (which were formulated 
from the interim meeting held on May 6th):

1. In regards to draft-ietf-kitten-sasl-oauth,RFC 6616, and RFC 6595;do 
we allow for GS2 mechanisms that don't providemutual authentication? 
This would entail changing the GS2 specification (RFC 5801) to relax 
this constraint.

a. Yes
b. No
c. Don't careor need more information

2. Do we allow the IAKERB draft (draft-ietf-kitten-iakerb) to pull in 
the finished message text from the PKU2U draft (draft-zhu-pku2u)?  
Subsequently, if the PKU2U draftis progressed, it will make a normative 
reference to the IAKERB draft.

a. Yes
b. No
c. Don't careor need more information

3. In regards todraft-williams-kitten-channel-bound-flag; are you in 
favor of using the NULL contextsolution for the channel bound 
indicatoras opposed to a new set credential API?

a. Yes
b. No
c. Don't careor need more information

Please provide your input before May 29th.Thank you.

Shawn Emery.
kitten co-chair
--

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<html>
  <head>

    <meta http-equiv="content-type" content="text/html; charset=ISO-8859-1">
  </head>
  <body bgcolor="#FFFFFF" text="#000000">
    <br>
    <big><tt>The WG is making the following consensus calls (which were
        formulated from the interim meeting held on May 6th):</tt></big><br>
    <div class="moz-forward-container"><font size="+1"><tt><font
            size="+1"><font size="+1"> <br>
              <font size="+1">1. In regards to
                draft-ietf-kitten-sasl-oauth<font size="+1">,<font
                    size="+1"> </font>RFC 6616, and RFC 6595</font>;<font
                  size="+1"> <font size="+1">d</font></font>o we allow
                for GS2 <font size="+1">mechanisms that don't provide<font
                    size="+1"> mutual authentication<font size="+1">?&nbsp;
                      This would <font size="+1">e<font size="+1">ntail</font>
                        changing the GS2 specification (RFC 5801) to
                        relax this constraint.</font><br>
                      <br>
                      <font size="+1"><font size="+1"><font size="+1">a.
                            Yes</font><br>
                          b. No<br>
                          <font size="+1">c. Don't care<font size="+1">
                              or </font>need more informati<font
                              size="+1">on</font></font><br>
                        </font></font></font></font></font>&nbsp;</font><br>
              2<font size="+1">. Do we allow the IAKERB </font>draft
              (draft-ietf-kitten-iakerb) to pull in <font size="+1">the
                finished message text from <font size="+1">the PKU2U
                  draft (draft-zhu-pku2u)?&nbsp; Subsequently, <font
                    size="+1">if the</font> PKU<font size="+1">2U</font>
                  draft<font size="+1"> </font>is progressed<font
                    size="+1">,</font> it will make a normative
                  reference to the IAKERB draft.<br>
                  <br>
                  <font size="+1"><font size="+1">a. Yes<br>
                      <font size="+1">b. No<br>
                        <font size="+1">c. Don't care<font size="+1"> <font
                              size="+1">or </font></font>need more
                          information<br>
                          <br>
                          <font size="+1"><font size="+1">3. <font
                                size="+1">In regards to<font size="+1">
                                </font>draft-williams-kitten-channel-bound-flag;

                                <font size="+1">a</font>re you in favor
                                of using the NULL context<font size="+1">
                                  solution for the channel bound
                                  indicator<font size="+1"> as opposed <font
                                      size="+1">to a new set credential
                                      API</font></font>?<br>
                                  <br>
                                  <font size="+1">a. Yes<br>
                                    <font size="+1">b. No<br>
                                      <font size="+1">c<font size="+1">.
                                          Don't care<font size="+1"> or
                                          </font>need more information</font></font></font></font></font></font></font></font></font></font></font></font></font></font><font
                size="+1"><font size="+1"><br>
                  <br>
                  <font size="+1">Please pr<font size="+1">ovi<font
                        size="+1">de your input before May 29th.<font
                          size="+1">&nbsp; </font>Thank you.<br>
                        <br>
                      </font></font></font> <font size="+1">Shawn
                    Emery.<br>
                    <font size="+1">kitten co-chair</font><br>
                    <font size="+1">--</font></font></font></font></font></font></tt></font><br>
    </div>
  </body>
</html>

--------------090104010106040304090708--

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From: Kelley Burgin <kwburgi@tycho.ncsc.mil>
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Thanks for your comments, my responses inline below. Basically, I'm  
happy to make the requested changes and have some proposed solutions  
for when the plaintext length is less than the blocksize.

Kelley

> I think this is in fairly good shape. My comments seem to mostly fall
> into two categories:
>
> 1) As chair I'm requesting that this document make no reference to
> terminology or concepts introduced in the simplified profile in RFC
> 3961.
> For the most part I'd expect this spec to refer only to RFC 3961
> sections 3 and 4.
>
[kwb] No problem.

> 2) I recommend that the editors minimize references to RFC 3962; in
> general repeating text from RFC 3962 is probably better than  
> references.
> This is a recommendation, not a requirement for progression; if the
> editors consider the issue and believe that some references to RFC  
> 3962
> improve clarity or minimize the probability of specification or
> implementation error, I'll be happy with that.
>
[kwb] No problem.
>
> The salt input to string_to_key is not under the control of a
> specification of an RFC 3961 enctype.
> It's inappropriate to place restrictions on the salt in this
> specification.
> Operationally what you may want is to encourage KDCs to include 128- 
> bits
> of randomness in the salt they use.
> That doesn't belong as part of the encryption type specification; it  
> may
> be appropriate in the same document, clearly separated.
>
> However, I think there are some issues related to keying services that
> tend to come up if the salt contains random data. I know the MIT folks
> explored this; I don't remember all the conclusions.
>
> If this property is important, you'll almost certainly want to explore
> advantages attackers could gain by causing a client to use the default
> Kerberos salt--that is, just the principal and realm.  If we don't end
> up liking the implications of that analysis we'll need to look at
> changes broader in scope than are appropriate for an enctype
> specification.
>
[kwb] Are you ok with "SHOULD include 128-bits of random"?

>
> Section 5:
>
>
> You seem to be using the function dr(), defined as part of the
> simplified profile in RFC 3961, but your definition is different than
> that in RFC 3961.  I find this notation confusing and would recommend
> against adopting notation from the simplified profile.
>
> Similarly, calling the key usage input to the key derivation n is
> notation from the simplified profile, not from section 3 of RFC 3961  
> and
> is highly confusing.
>
[kwb] I'll change this.
>
> section 6:
>
> The use of notation from the simplified profile is really problematic
> here.
>
> I think using cE, D and m is fine. I just think it would be  
> desirable to
> define them yourself rather than referencing the simplified profile
> definitions.
>
> I think I'd like to hear responses to these comments before deciding
> whether we're ready for working group last call.
>
>
> ------------------------------
>
> Date: Tue, 14 May 2013 19:00:26 -0400
> From: Greg Hudson <ghudson@MIT.EDU>
> To: Sam Hartman <hartmans-ietf@mit.edu>
> Cc: kitten@ietf.org
> Subject: Re: [kitten] Comments on
> 	draft-ietf-kitten-aes-cts-hmac-sha2-00
> Message-ID: <5192C20A.6040907@mit.edu>
> Content-Type: text/plain; charset=ISO-8859-1
>
> I have an additional comment:
>
> Section 6 notes that "[SP800-38A+] requires the plaintext length to be
> greater than or equal to the block size" but gives no guidance on what
> to do if the input is smaller than that.  This seems like a pretty
> serious problem.

[kwb] CTS won't work, so two work arounds are:
1. Pad the plaintext to a block length, but this brings back issues  
with the ciphertext length being greater than plaintext length.
2. Use a different mode, counter mode for example (only in this  
special case). Encrypt the IV and xor the result with the plaintext  
(padded with zeros). Output the appropriate partial ciphertext so  
there's no expansion.




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>>>>> "Kelley" == Kelley Burgin <kwburgi@tycho.ncsc.mil> writes:
    Kelley> [kwb] Are you ok with "SHOULD include 128-bits of random"?

Not really.  That feels like ignoring an important issue.  The point you
bring up about salt seems significant and I think deserves more than a
sentence, especially a SHOULD without qualifications.

I'd like to first understand from Greg or Ken or whoever looked at
random salts at MIT what the complexities are.
Then  I'd like to better understand how you want this requirement
enforced and what attacks you are worried about.

At that point I think we can propose some text for a new section.

--------------------

I'd like to ask the WG whether we think the less-than-a-block issue is a
practical problem or whether it's just a completeness issue.

If we don't expect either GSS-API or Kerberos messages to generate
inputs less than a block, then I think having "trailing crypto garbage,"
(ciphertext length greater than plaintext length) in that one case might
be fine.

Thoughts?

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On 05/16/2013 11:26 AM, Sam Hartman wrote:
>>>>>> "Kelley" == Kelley Burgin <kwburgi@tycho.ncsc.mil> writes:
>     Kelley> [kwb] Are you ok with "SHOULD include 128-bits of random"?
> 
> Not really.  That feels like ignoring an important issue.  The point you
> bring up about salt seems significant and I think deserves more than a
> sentence, especially a SHOULD without qualifications.

I agree with Sam here.  An RFC 3961 enctype defines a (random) function,
not a set of constraints on the inputs.  This seems like fodder for the
suiteb draft or something else.

> I'd like to first understand from Greg or Ken or whoever looked at
> random salts at MIT what the complexities are.

Here's what I ran into when trying to make random salts the default in
MIT krb5:

* Password history checking stops working as we currently implement it
in MIT krb5, and the obvious alternative makes changing passwords more
computationally expensive for kadmind.

* ktutil's add_entry command assumes the default salt.  A similar
problem applies when keying Windows services, if I understand how that
normally works.

* Cross-realm TGTs are currently managed by entering the same password
at two KDCs to get the same keys.  If each KDC uses a random salt, they
won't have the same keys.

All of these can be mitigated, but it adds up to a substantial project.
 We added support for random salts in 1.10, but not by default (and it
only uses a non-configurable 64 random bits at the moment, but that's a
simple change).

> I'd like to ask the WG whether we think the less-than-a-block issue is a
> practical problem or whether it's just a completeness issue.

It would be a serious practical problem if an enctype implementation was
expected to just fail on inputs less than 16 bytes.  I don't know if it
would be a practical problem to have ciphertext expansion for a small
input.  I suspect it wouldn't be a problem for MIT krb5 since we're used
to it with DES and DES3 (although not with CFX in GSSAPI).

I tried running our test suite with a 16-byte plaintext minimum to
identify small messages, but it only got as far as encrypting key data
during KDB setup.  That's not a PDU so it's not terribly interesting.

I'm interested in Kelley's idea of using CTR with the random IV as the
counter.  Obviously an IV collision would expose the XOR of the
plaintexts of the colliding blocks, but I think that's no worse than CBC
(a colliding cipher block exposes the XOR of the plaintexts of the
preceding blocks, IIRC).


From kwburgi@tycho.ncsc.mil  Fri May 17 06:44:17 2013
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Even though I see value in adding random to the salt, I don't think it  
warrants taking on a substantial project. Any objections to taking out  
the requirement for random in the salt, and adding some text to the  
effect of "If NIST guidance to include 128 bits of random in the salt  
is followed, be aware of these issues..." Also make a note that the  
random would need to be passed to the client in some appropriate  
padata field?

Kelley

On May 16, 2013, at 12:36 PM, Greg Hudson wrote:

> On 05/16/2013 11:26 AM, Sam Hartman wrote:
>>>>>>> "Kelley" == Kelley Burgin <kwburgi@tycho.ncsc.mil> writes:
>>    Kelley> [kwb] Are you ok with "SHOULD include 128-bits of random"?
>>
>> Not really.  That feels like ignoring an important issue.  The  
>> point you
>> bring up about salt seems significant and I think deserves more  
>> than a
>> sentence, especially a SHOULD without qualifications.
>
> I agree with Sam here.  An RFC 3961 enctype defines a (random)  
> function,
> not a set of constraints on the inputs.  This seems like fodder for  
> the
> suiteb draft or something else.
>
>> I'd like to first understand from Greg or Ken or whoever looked at
>> random salts at MIT what the complexities are.
>
> Here's what I ran into when trying to make random salts the default in
> MIT krb5:
>
> * Password history checking stops working as we currently implement it
> in MIT krb5, and the obvious alternative makes changing passwords more
> computationally expensive for kadmind.
>
> * ktutil's add_entry command assumes the default salt.  A similar
> problem applies when keying Windows services, if I understand how that
> normally works.
>
> * Cross-realm TGTs are currently managed by entering the same password
> at two KDCs to get the same keys.  If each KDC uses a random salt,  
> they
> won't have the same keys.
>
> All of these can be mitigated, but it adds up to a substantial  
> project.
> We added support for random salts in 1.10, but not by default (and it
> only uses a non-configurable 64 random bits at the moment, but  
> that's a
> simple change).
>
>> I'd like to ask the WG whether we think the less-than-a-block issue  
>> is a
>> practical problem or whether it's just a completeness issue.
>
> It would be a serious practical problem if an enctype implementation  
> was
> expected to just fail on inputs less than 16 bytes.  I don't know if  
> it
> would be a practical problem to have ciphertext expansion for a small
> input.  I suspect it wouldn't be a problem for MIT krb5 since we're  
> used
> to it with DES and DES3 (although not with CFX in GSSAPI).
>
> I tried running our test suite with a 16-byte plaintext minimum to
> identify small messages, but it only got as far as encrypting key data
> during KDB setup.  That's not a PDU so it's not terribly interesting.
>
> I'm interested in Kelley's idea of using CTR with the random IV as the
> counter.  Obviously an IV collision would expose the XOR of the
> plaintexts of the colliding blocks, but I think that's no worse than  
> CBC
> (a colliding cipher block exposes the XOR of the plaintexts of the
> preceding blocks, IIRC).
>


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Cc: kitten@ietf.org, Sam Hartman <hartmans-ietf@mit.edu>
Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On 05/17/2013 09:47 AM, Kelley Burgin wrote:
> Even though I see value in adding random to the salt, I don't think it
> warrants taking on a substantial project. Any objections to taking out
> the requirement for random in the salt, and adding some text to the
> effect of "If NIST guidance to include 128 bits of random in the salt is
> followed, be aware of these issues..." Also make a note that the random
> would need to be passed to the client in some appropriate padata field?

I'm opposed to having any text in an encryption type specification about
the contents of the salt.  An enctype implementation accepts the salt as
input from a higher layer; it does not choose what goes into the salt.

An RFC can contain multiple things (an enctype spec and also some text
about salts), but they should be clearly delineated, and I'm not sure
what this RFC would need to say about salts which isn't already stated
in RFC 4120.


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To: Kelley Burgin <kwburgi@tycho.ncsc.mil>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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>>>>> "Kelley" == Kelley Burgin <kwburgi@tycho.ncsc.mil> writes:

    Kelley> Even though I see value in adding random to the salt, I
    Kelley> don't think it warrants taking on a substantial project. Any
    Kelley> objections to taking out the requirement for random in the
    Kelley> salt, and adding some text to the effect of "If NIST
    Kelley> guidance to include 128 bits of random in the salt is
    Kelley> followed, be aware of these issues..." Also make a note that
    Kelley> the random would need to be passed to the client in some
    Kelley> appropriate padata field?

it sounds like you and Greg might both be happy with a new section in
this document discussing random salts, and pointing out the issues.
Greg asks what there is to say beyond RFC 4120?
I think the big thing would be to give advice on how to figure out the
salt of a service or cross-realm key.

If we can find guidance for how implementations should approach that
would it be valuable to document that guidance here?

From kwburgi@tycho.ncsc.mil  Fri May 17 07:22:29 2013
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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We do have text about prepending the enctype name to the salt, which I  
think is important (although I guess this is technically saltp but  
still used as the "salt" in PBKDF). Are you opposed to random in the  
salt in the test vectors?

On May 17, 2013, at 10:00 AM, Greg Hudson wrote:

> On 05/17/2013 09:47 AM, Kelley Burgin wrote:
>> Even though I see value in adding random to the salt, I don't think  
>> it
>> warrants taking on a substantial project. Any objections to taking  
>> out
>> the requirement for random in the salt, and adding some text to the
>> effect of "If NIST guidance to include 128 bits of random in the  
>> salt is
>> followed, be aware of these issues..." Also make a note that the  
>> random
>> would need to be passed to the client in some appropriate padata  
>> field?
>
> I'm opposed to having any text in an encryption type specification  
> about
> the contents of the salt.  An enctype implementation accepts the  
> salt as
> input from a higher layer; it does not choose what goes into the salt.
>
> An RFC can contain multiple things (an enctype spec and also some text
> about salts), but they should be clearly delineated, and I'm not sure
> what this RFC would need to say about salts which isn't already stated
> in RFC 4120.
>


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To: Kelley Burgin <kwburgi@tycho.ncsc.mil>
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>>>>> "Kelley" == Kelley Burgin <kwburgi@tycho.ncsc.mil> writes:

    Kelley> We do have text about prepending the enctype name to the
    Kelley> salt, which I think is important (although I guess this is
    Kelley> technically saltp but still used as the "salt" in
    Kelley> PBKDF). 

I think that the way prepending the enctype name to the salt is done is
fine.
it's entirely internal to the crypto system.

    Kelley> Are you opposed to random in the salt in the test
    Kelley> vectors?

As an individual I think that's fine.

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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On 05/17/2013 10:25 AM, Kelley Burgin wrote:
> We do have text about prepending the enctype name to the salt, which I
> think is important (although I guess this is technically saltp but still
> used as the "salt" in PBKDF).

The distinction is important.  The salt value arrives as an input from
the RFC 4120 layer.  What the enctype feeds into PBKDF2 is an internal
detail of the enctype.  (But an enctype cannot add random data to the
input salt and feed that to PBKDF2, because string-to-key is not a
random function.)

> Are you opposed to random in the salt in the test vectors?

Not at all.  Programs which verify test vectors can feed in whatever
salt is required.  However, do note that RFC 3961 restricts salts to
valid UTF-8 sequences.


From kwburgi@tycho.ncsc.mil  Fri May 17 09:36:18 2013
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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To be clear, in response to Sam's earlier question, are you against a  
section discussing random salts which discusses cross realm issues?

Thanks for reminding me about the UTF-8 restriction.

On May 17, 2013, at 10:29 AM, Greg Hudson wrote:

> On 05/17/2013 10:25 AM, Kelley Burgin wrote:
>> We do have text about prepending the enctype name to the salt,  
>> which I
>> think is important (although I guess this is technically saltp but  
>> still
>> used as the "salt" in PBKDF).
>
> The distinction is important.  The salt value arrives as an input from
> the RFC 4120 layer.  What the enctype feeds into PBKDF2 is an internal
> detail of the enctype.  (But an enctype cannot add random data to the
> input salt and feed that to PBKDF2, because string-to-key is not a
> random function.)
>
>> Are you opposed to random in the salt in the test vectors?
>
> Not at all.  Programs which verify test vectors can feed in whatever
> salt is required.  However, do note that RFC 3961 restricts salts to
> valid UTF-8 sequences.
>


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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On 05/17/2013 12:39 PM, Kelley Burgin wrote:
> To be clear, in response to Sam's earlier question, are you against a
> section discussing random salts which discusses cross realm issues?

I am not raising an objection to such a section if it is clearly
separate from the enctype specification.  (But I also don't see the need
for it, and if there is a need, I wonder if it would fit better in the
suiteb draft.)


From kwburgi@tycho.ncsc.mil  Fri May 17 10:24:27 2013
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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I agree it might fit better in a different document, but Suite B does  
not use password based authentication (we require pkinit). The text we  
have on passwords is to be a complete enctype, that provides a high  
level of security independent of network security policy (e.g.  
password strength requirements).

I'm happy to include a section in this draft on random salts, if there  
is a need as you say, and if we can come up with a solution to cross  
realm problems (I don't have one).

On May 17, 2013, at 12:52 PM, Greg Hudson wrote:

> On 05/17/2013 12:39 PM, Kelley Burgin wrote:
>> To be clear, in response to Sam's earlier question, are you against a
>> section discussing random salts which discusses cross realm issues?
>
> I am not raising an objection to such a section if it is clearly
> separate from the enctype specification.  (But I also don't see the  
> need
> for it, and if there is a need, I wonder if it would fit better in the
> suiteb draft.)
>


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Date: Mon, 20 May 2013 15:10:52 -0500
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From: Nico Williams <nico@cryptonector.com>
To: Greg Hudson <ghudson@mit.edu>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Tue, May 14, 2013 at 6:00 PM, Greg Hudson <ghudson@mit.edu> wrote:
> I have an additional comment:
>
> Section 6 notes that "[SP800-38A+] requires the plaintext length to be
> greater than or equal to the block size" but gives no guidance on what
> to do if the input is smaller than that.  This seems like a pretty
> serious problem.
>
> The RFC 3962 enctypes do not have this problem because they use a
> confounder, which adds a block of input.  They did have to specify what
> to do when the input length is 0, such that the cipher plaintext is
> exactly one block.

I agree, this needs to be resolved.

It also makes me wonder why no confounder.  I don't think we must have
confounders (or CTS), and I'd not insist on having them, but I'm
curious as to why not keep using confounders.  So far my best guess is
that confounding increases the *plaintext* size (not just the
ciphertext), and this might cause performance problems in some
hardware-assisted implementations.

I'm not sure what, if anything, we lose by having an IV instead of a
confounder.  Eavesdroppers get to see the IV, but not the confounder's
plaintext, and this presumably leaks some information about the
sender's entropy, but it's not clear that we should care, since we
assume [and very much depend on having] a decent enough [P]RNG with
decent enough seeding [in the PRNG case].  Active attackers also get
to modify the IV, but they get to modify the confounder, and any other
bit of ciphertext and so on, so this is not an issue.

As for what to do when the input is shorter than a full ciphertext
block, there are some options.  The two most obvious ones are: pad, or
confound.  My preference would be to confound in this case.  Kerberos
itself never really needs to encrypt plaintexts shorter than 128 bits
today, IIRC, but the GSS mechanism has to support shorter plaintexts,
and Kerberos may have to some day for all we know.

Nico
--

From jhutz@cmu.edu  Mon May 20 13:31:43 2013
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Mon, 2013-05-20 at 15:10 -0500, Nico Williams wrote:

> As for what to do when the input is shorter than a full ciphertext
> block, there are some options.  The two most obvious ones are: pad, or
> confound.  My preference would be to confound in this case.  Kerberos
> itself never really needs to encrypt plaintexts shorter than 128 bits
> today, IIRC, but the GSS mechanism has to support shorter plaintexts,
> and Kerberos may have to some day for all we know.

RFC3961 also gets used by other protocols, both within and outside the
IETF.  Some of these do or may include plaintexts shorter than 16 bytes,
so IMHO, failing to deal with such short plaintexts is definitely a
problem.

-- Jeff


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On Thu, May 16, 2013 at 10:26 AM, Sam Hartman <hartmans-ietf@mit.edu> wrote:
>>>>>> "Kelley" == Kelley Burgin <kwburgi@tycho.ncsc.mil> writes:
>     Kelley> [kwb] Are you ok with "SHOULD include 128-bits of random"?
>
> Not really.  That feels like ignoring an important issue.  The point you
> bring up about salt seems significant and I think deserves more than a
> sentence, especially a SHOULD without qualifications.
>
> I'd like to first understand from Greg or Ken or whoever looked at
> random salts at MIT what the complexities are.
> Then  I'd like to better understand how you want this requirement
> enforced and what attacks you are worried about.

In theory randomized salts should have little impact.  In practice
there are least some moderate impacts (e.g., ktutil-type applications
should not assume a salt when generating a keytab entry from a
password).

I understand the value of randomizing salts, but having *any* salt
gets us the most important feature: defeating rainbow table
precomputation (by requiring per-principal rainbow tables).

Nico
--

From tlyu@mit.edu  Mon May 20 15:37:12 2013
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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Kelley Burgin <kwburgi@tycho.ncsc.mil> writes:

> [kwb] CTS won't work, so two work arounds are:
> 1. Pad the plaintext to a block length, but this brings back issues
> with the ciphertext length being greater than plaintext length.
> 2. Use a different mode, counter mode for example (only in this
> special case). Encrypt the IV and xor the result with the plaintext
> (padded with zeros). Output the appropriate partial ciphertext so
> there's no expansion.

I think CTS will work if you are willing to modify the "IV" sent when
the plaintext length is less than or equal to the block size;
basically treat the IV as the next to last block of CBC ciphertext,
truncating it to the length of the plaintext, and send the final block
of CBC ciphertext as the "IV".

I'm not sure how to adapt this approach to the current document,
because the current approach doesn't send the IV, but rather sends the
nonce from which the IV is derived.

From nico@cryptonector.com  Mon May 20 16:13:45 2013
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From: Nico Williams <nico@cryptonector.com>
To: Tom Yu <tlyu@mit.edu>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Mon, May 20, 2013 at 5:37 PM, Tom Yu <tlyu@mit.edu> wrote:
> Kelley Burgin <kwburgi@tycho.ncsc.mil> writes:
>
>> [kwb] CTS won't work, so two work arounds are:
>> 1. Pad the plaintext to a block length, but this brings back issues
>> with the ciphertext length being greater than plaintext length.
>> 2. Use a different mode, counter mode for example (only in this
>> special case). Encrypt the IV and xor the result with the plaintext
>> (padded with zeros). Output the appropriate partial ciphertext so
>> there's no expansion.
>
> I think CTS will work if you are willing to modify the "IV" sent when
> the plaintext length is less than or equal to the block size;
> basically treat the IV as the next to last block of CBC ciphertext,
> truncating it to the length of the plaintext, and send the final block
> of CBC ciphertext as the "IV".
>
> I'm not sure how to adapt this approach to the current document,
> because the current approach doesn't send the IV, but rather sends the
> nonce from which the IV is derived.

I don't see the problem.  In the short-plaintext case we'd have:

   C = E(Ke, N | plaintext, cipherstate)
   H = HMAC(Ki, C)
   ciphertext = C

and corresponding change to the decrypt side:

   (C, H) = ciphertext
   if (H != HMAC(Ki, C)[1..h])
      stop, report error
   IV = cipherstate
   (N, P) = D(Ke, C, IV)
   cipherState = N

I remembered a reason not to confound whenever possible: performance
-- fewer encryption/decryption operations.

Nico
--

From hotz@jpl.nasa.gov  Mon May 20 16:46:26 2013
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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Obviously off-topic, but I've advocated for a "keytab import" =
administrative function as a way to avoid retyping passwords in this =
case.  Yeah, yeah, "write it yourself, it's open-source", I know.

On May 16, 2013, at 9:36 AM, Greg Hudson <ghudson@MIT.EDU> wrote:

> * Cross-realm TGTs are currently managed by entering the same password
> at two KDCs to get the same keys.  If each KDC uses a random salt, =
they
> won't have the same keys.

------------------------------------------------------
The opinions expressed in this message are mine,
not those of Caltech, JPL, NASA, or the US Government.
Henry.B.Hotz@jpl.nasa.gov, or hbhotz@oxy.edu


From nico@cryptonector.com  Mon May 20 17:04:22 2013
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Subject: [kitten] OT: ktutil and x-realm keys (Re: Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00)
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On Mon, May 20, 2013 at 6:46 PM, Henry B. Hotz <hotz@jpl.nasa.gov> wrote:
> On May 16, 2013, at 9:36 AM, Greg Hudson <ghudson@MIT.EDU> wrote:
>> * Cross-realm TGTs are currently managed by entering the same password
>> at two KDCs to get the same keys.  If each KDC uses a random salt, they
>> won't have the same keys.
>
> Obviously off-topic, but I've advocated for a "keytab import" administrative function as a way to avoid retyping passwords in this case.  Yeah, yeah, "write it yourself, it's open-source", I know.

I don't think that's the best way to implement this.  As long as we
must have password-based x-realm keys the way it should work is that
one admin creates an x-realm princ on on realm, then the other realm's
admin does an AS exchange to fetch the salt (and other s2kparams) and
validate the password they've been told on the phone/whatever, then
the key gets added to that realm.  This is, also, how password-based
keys should be added to keytabs (to fetch the salt and other
s2kparams).

But this is off-topic, and also off-topic: we really need
password-authenticated DH-exchanged x-realm keys and PKI-authenticated
DH-exchanged x-realm keys.  I.e., PKCROSS.

Nico
--

From tlyu@mit.edu  Mon May 20 17:23:24 2013
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To: Nico Williams <nico@cryptonector.com>
References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com>
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Date: Mon, 20 May 2013 20:21:40 -0400
In-Reply-To: <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> (Nico Williams's message of "Mon, 20 May 2013 18:13:38 -0500")
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Nico Williams <nico@cryptonector.com> writes:

> On Mon, May 20, 2013 at 5:37 PM, Tom Yu <tlyu@mit.edu> wrote:
>> Kelley Burgin <kwburgi@tycho.ncsc.mil> writes:
>>
>>> [kwb] CTS won't work, so two work arounds are:
>>> 1. Pad the plaintext to a block length, but this brings back issues
>>> with the ciphertext length being greater than plaintext length.
>>> 2. Use a different mode, counter mode for example (only in this
>>> special case). Encrypt the IV and xor the result with the plaintext
>>> (padded with zeros). Output the appropriate partial ciphertext so
>>> there's no expansion.
>>
>> I think CTS will work if you are willing to modify the "IV" sent when
>> the plaintext length is less than or equal to the block size;
>> basically treat the IV as the next to last block of CBC ciphertext,
>> truncating it to the length of the plaintext, and send the final block
>> of CBC ciphertext as the "IV".
>>
>> I'm not sure how to adapt this approach to the current document,
>> because the current approach doesn't send the IV, but rather sends the
>> nonce from which the IV is derived.
>
> I don't see the problem.  In the short-plaintext case we'd have:
>
>    C = E(Ke, N | plaintext, cipherstate)
>    H = HMAC(Ki, C)
>    ciphertext = C

That's not quite right, unless you're redefining E.  If E is
SP800-38A+ "CBC-CS3", it doesn't really work unless len(plaintext) is
greater than the blocksize.  We can still send a truncated nonce
instead of a truncated IV, because we can recover the entire IV on
decryption.

plen = len(plaintext)
if plen < blocksize:
  C = Enc-CBC(Ke, plaintext | nullpad, IV)
  N1 = C[1..blocksize]
  C1 = N[1..plen]
  H = HMAC(Ki, N1 | C1)
  ciphertext = N1 | C1 | H[1..h]

From nico@cryptonector.com  Mon May 20 17:56:36 2013
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References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu>
Date: Mon, 20 May 2013 19:56:23 -0500
Message-ID: <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com>
From: Nico Williams <nico@cryptonector.com>
To: Tom Yu <tlyu@mit.edu>
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Cc: kitten@ietf.org, Sam Hartman <hartmans-ietf@mit.edu>
Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Mon, May 20, 2013 at 7:21 PM, Tom Yu <tlyu@mit.edu> wrote:
> Nico Williams <nico@cryptonector.com> writes:
>
>> On Mon, May 20, 2013 at 5:37 PM, Tom Yu <tlyu@mit.edu> wrote:
>>> Kelley Burgin <kwburgi@tycho.ncsc.mil> writes:
>>>
>>>> [kwb] CTS won't work, so two work arounds are:
>>>> 1. Pad the plaintext to a block length, but this brings back issues
>>>> with the ciphertext length being greater than plaintext length.
>>>> 2. Use a different mode, counter mode for example (only in this
>>>> special case). Encrypt the IV and xor the result with the plaintext
>>>> (padded with zeros). Output the appropriate partial ciphertext so
>>>> there's no expansion.
>>>
>>> I think CTS will work if you are willing to modify the "IV" sent when
>>> the plaintext length is less than or equal to the block size;
>>> basically treat the IV as the next to last block of CBC ciphertext,
>>> truncating it to the length of the plaintext, and send the final block
>>> of CBC ciphertext as the "IV".
>>>
>>> I'm not sure how to adapt this approach to the current document,
>>> because the current approach doesn't send the IV, but rather sends the
>>> nonce from which the IV is derived.
>>
>> I don't see the problem.  In the short-plaintext case we'd have:
>>
>>    C = E(Ke, N | plaintext, cipherstate)
>>    H = HMAC(Ki, C)
>>    ciphertext = C
>
> That's not quite right, unless you're redefining E.  If E is
> SP800-38A+ "CBC-CS3", it doesn't really work unless len(plaintext) is
> greater than the blocksize.  We can still send a truncated nonce
> instead of a truncated IV, because we can recover the entire IV on
> decryption.

Here E() operates on a plaintext 16-31 bytes long: E | P.  There's no problem.

From tlyu@mit.edu  Mon May 20 20:59:00 2013
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To: Nico Williams <nico@cryptonector.com>
References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com>
From: Tom Yu <tlyu@MIT.EDU>
Date: Mon, 20 May 2013 23:58:41 -0400
In-Reply-To: <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> (Nico Williams's message of "Mon, 20 May 2013 19:56:23 -0500")
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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Nico Williams <nico@cryptonector.com> writes:

> On Mon, May 20, 2013 at 7:21 PM, Tom Yu <tlyu@mit.edu> wrote:
>> Nico Williams <nico@cryptonector.com> writes:
>>
>>> On Mon, May 20, 2013 at 5:37 PM, Tom Yu <tlyu@mit.edu> wrote:
>>>> Kelley Burgin <kwburgi@tycho.ncsc.mil> writes:
>>>>
>>>>> [kwb] CTS won't work, so two work arounds are:
>>>>> 1. Pad the plaintext to a block length, but this brings back issues
>>>>> with the ciphertext length being greater than plaintext length.
>>>>> 2. Use a different mode, counter mode for example (only in this
>>>>> special case). Encrypt the IV and xor the result with the plaintext
>>>>> (padded with zeros). Output the appropriate partial ciphertext so
>>>>> there's no expansion.
>>>>
>>>> I think CTS will work if you are willing to modify the "IV" sent when
>>>> the plaintext length is less than or equal to the block size;
>>>> basically treat the IV as the next to last block of CBC ciphertext,
>>>> truncating it to the length of the plaintext, and send the final block
>>>> of CBC ciphertext as the "IV".
>>>>
>>>> I'm not sure how to adapt this approach to the current document,
>>>> because the current approach doesn't send the IV, but rather sends the
>>>> nonce from which the IV is derived.
>>>
>>> I don't see the problem.  In the short-plaintext case we'd have:
>>>
>>>    C = E(Ke, N | plaintext, cipherstate)
>>>    H = HMAC(Ki, C)
>>>    ciphertext = C
>>
>> That's not quite right, unless you're redefining E.  If E is
>> SP800-38A+ "CBC-CS3", it doesn't really work unless len(plaintext) is
>> greater than the blocksize.  We can still send a truncated nonce
>> instead of a truncated IV, because we can recover the entire IV on
>> decryption.
>
> Here E() operates on a plaintext 16-31 bytes long: E | P.  There's no problem.

I think you mean the plaintext is N | plaintext.  It sounds like
you're making the short-plaintext encryption change to using a
confounder, which the current document seems to deliberately avoid.

From nico@cryptonector.com  Mon May 20 21:45:51 2013
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References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu>
Date: Mon, 20 May 2013 23:45:43 -0500
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From: Nico Williams <nico@cryptonector.com>
To: Tom Yu <tlyu@mit.edu>
Content-Type: text/plain; charset=UTF-8
Cc: kitten@ietf.org, Sam Hartman <hartmans-ietf@mit.edu>
Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Mon, May 20, 2013 at 10:58 PM, Tom Yu <tlyu@mit.edu> wrote:
> Nico Williams <nico@cryptonector.com> writes:
>> On Mon, May 20, 2013 at 7:21 PM, Tom Yu <tlyu@mit.edu> wrote:
>>> Nico Williams <nico@cryptonector.com> writes:
>>>> I don't see the problem.  In the short-plaintext case we'd have:
>>>>
>>>>    C = E(Ke, N | plaintext, cipherstate)
>>>>    H = HMAC(Ki, C)
>>>>    ciphertext = C
>>>
>>> That's not quite right, unless you're redefining E.  If E is
>>> SP800-38A+ "CBC-CS3", it doesn't really work unless len(plaintext) is
>>> greater than the blocksize.  We can still send a truncated nonce
>>> instead of a truncated IV, because we can recover the entire IV on
>>> decryption.
>>
>> Here E() operates on a plaintext 16-31 bytes long: E | P.  There's no problem.
>
> I think you mean the plaintext is N | plaintext.  It sounds like

That's what I wrote, yes :)

> you're making the short-plaintext encryption change to using a
> confounder, which the current document seems to deliberately avoid.

I don't know why the current document avoids confounding, not even
whether it does so deliberately or by accident -- the topic is not
addressed.  Section 1 addresses differences from aes-cts-hmac-sha-1,
but does not cover this one; it should.

Nico
--

From kwburgi@tycho.ncsc.mil  Tue May 21 09:15:18 2013
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Both Tom's and Nico's short-plaintext schemes miss something I'm  
looking for: the presence of the IV in the MAC computation. Otherwise  
the MAC value H is always the same for a given C (output of the  
encryption operation).

In general, we want to encrypt-then-mac, include the IV directly in  
the MAC computation and on the receiving end check the MAC before  
decryption (to save decrypting a long message only to find out later  
that the MAC doesn't verify). I'm probably fine with a scheme that  
doesn't do the last two in short-plaintext cases (like Tom's and  
Nico's). However, to achieve all three, the nonce needs to be sent as  
part of the ciphertext.

Here are my comments on the two proposed short-plaintext schemes:

In Tom's scheme for short-plaintext cases, it seems that duplicate  
information is being sent, if I understand correctly: isn't C1 a  
subset of the bits of N1? If so, it would be useful to include part of  
the IV in the MAC computation instead of C1 to diversify the MAC  
values for a given C.

Tom's:
[
plen = len(plaintext)
if plen < blocksize:
  C = Enc-CBC(Ke, plaintext | nullpad, IV)
  N1 = C[1..blocksize]
  C1 = N[1..plen]
  H = HMAC(Ki, N1 | C1)
  ciphertext = N1 | C1 | H[1..h]
]

could change to (note the receiver has to decrypt first to recover the  
IV, then verify the MAC)

[
plen = len(plaintext)
if plen < blocksize:
  C = Enc-CBC(Ke, plaintext | nullpad, IV)
  IV* = IV[1..plen]     <-- don't truncate N1, use IV instead
H = HMAC(Ki, C | IV*)
ciphertext = C | IV* | H[1..h]
]

Nico's could also be modified to include the IV in the MAC  
computation, without expanding the ciphertext:

Nico's:
[
   C = E(Ke, N | plaintext, cipherstate)
   H = HMAC(Ki, C)
   ciphertext = C, H

and corresponding change to the decrypt side:

   (C, H) = ciphertext
   if (H != HMAC(Ki, C)[1..h])
      stop, report error
   IV = cipherstate
   (N, P) = D(Ke, C, IV)
   cipherState = N
]

could change to

[
   C = E(Ke, N | plaintext, cipherstate)
   H = HMAC(Ki, N | C)   <-- added nonce here
   ciphertext = C, H

decrypt

   (C, H) = ciphertext
   IV = cipherstate   <-- decrypt first to recover the nonce, then  
check MAC
   (N, P) = D(Ke, C, IV)
   if (H != HMAC(Ki, N | C)[1..h])
      stop, report error
   cipherState = N
]



On May 21, 2013, at 12:45 AM, Nico Williams wrote:

> On Mon, May 20, 2013 at 10:58 PM, Tom Yu <tlyu@mit.edu> wrote:
>> Nico Williams <nico@cryptonector.com> writes:
>>> On Mon, May 20, 2013 at 7:21 PM, Tom Yu <tlyu@mit.edu> wrote:
>>>> Nico Williams <nico@cryptonector.com> writes:
>>>>> I don't see the problem.  In the short-plaintext case we'd have:
>>>>>
>>>>>   C = E(Ke, N | plaintext, cipherstate)
>>>>>   H = HMAC(Ki, C)
>>>>>   ciphertext = C
>>>>
>>>> That's not quite right, unless you're redefining E.  If E is
>>>> SP800-38A+ "CBC-CS3", it doesn't really work unless  
>>>> len(plaintext) is
>>>> greater than the blocksize.  We can still send a truncated nonce
>>>> instead of a truncated IV, because we can recover the entire IV on
>>>> decryption.
>>>
>>> Here E() operates on a plaintext 16-31 bytes long: E | P.  There's  
>>> no problem.
>>
>> I think you mean the plaintext is N | plaintext.  It sounds like
>
> That's what I wrote, yes :)
>
>> you're making the short-plaintext encryption change to using a
>> confounder, which the current document seems to deliberately avoid.
>
> I don't know why the current document avoids confounding, not even
> whether it does so deliberately or by accident -- the topic is not
> addressed.  Section 1 addresses differences from aes-cts-hmac-sha-1,
> but does not cover this one; it should.
>
> Nico
> --



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On Mon, 2013-05-20 at 23:45 -0500, Nico Williams wrote:

> I don't know why the current document avoids confounding, not even
> whether it does so deliberately or by accident -- the topic is not
> addressed.  Section 1 addresses differences from aes-cts-hmac-sha-1,
> but does not cover this one; it should.

This is actually a problem.  Enctype design should be conservative; if
we're not going to have a confounder, I want to know why.

-- Jeff


From kwburgi@tycho.ncsc.mil  Tue May 21 10:02:14 2013
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Sorry - the reason was buried in the previous email:

In general, we want to
1. encrypt-then-mac,
2. include the IV directly in the MAC computation (so the MAC value H  
is different for the same output of the encryption operation C) and
3. on the receiving end check the MAC before decryption (to save  
decrypting a long message only to find out later that the MAC doesn't  
verify).

I'm probably fine with a scheme that doesn't do the last two in short- 
plaintext cases (like Tom's and Nico's). However, to achieve all  
three, the nonce needs to be sent as part of the ciphertext.

Also, we have coordinated, to the extent possible (the intended  
applications there don't have a problem with PKCS#5 padding), with  
draft-mcgrew-aead-aes-cbc-hmac-sha2

Kelley

On May 21, 2013, at 12:48 PM, Jeffrey Hutzelman wrote:

> On Mon, 2013-05-20 at 23:45 -0500, Nico Williams wrote:
>
>> I don't know why the current document avoids confounding, not even
>> whether it does so deliberately or by accident -- the topic is not
>> addressed.  Section 1 addresses differences from aes-cts-hmac-sha-1,
>> but does not cover this one; it should.
>
> This is actually a problem.  Enctype design should be conservative; if
> we're not going to have a confounder, I want to know why.
>
> -- Jeff
>
> _______________________________________________
> Kitten mailing list
> Kitten@ietf.org
> https://www.ietf.org/mailman/listinfo/kitten


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On Tue, 2013-05-21 at 13:05 -0400, Kelley Burgin wrote:
> Sorry - the reason was buried in the previous email:
> 
> In general, we want to
> 1. encrypt-then-mac,
> 2. include the IV directly in the MAC computation (so the MAC value H  
> is different for the same output of the encryption operation C) and
> 3. on the receiving end check the MAC before decryption (to save  
> decrypting a long message only to find out later that the MAC doesn't  
> verify).

OK; none of that explains why you do not prepend a random confounder to
the data to be encrypted.  I think you need to explain both why there is
no confounder and why it is not necessary.

-- Jeff


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Date: Tue, 21 May 2013 12:21:54 -0500
Message-ID: <CAK3OfOhfgfE65xrAsJy5iNLKuz8wNB8LikqHmiOYr5x8a7jmww@mail.gmail.com>
From: Nico Williams <nico@cryptonector.com>
To: Kelley Burgin <kwburgi@tycho.ncsc.mil>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Tue, May 21, 2013 at 11:18 AM, Kelley Burgin <kwburgi@tycho.ncsc.mil> wrote:
> Both Tom's and Nico's short-plaintext schemes miss something I'm looking
> for: the presence of the IV in the MAC computation. Otherwise the MAC value
> H is always the same for a given C (output of the encryption operation).

When confounding the ciphertext of the confounder is included in MAC
computation.  Why is this not sufficient?

From hartmans@mit.edu  Tue May 21 11:18:14 2013
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From: Sam Hartman <hartmans-ietf@mit.edu>
To: Nico Williams <nico@cryptonector.com>
References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu> <CAK3OfOiRsqC1RxbU96OGzOUj0=UEcQbXNKPrhBAgYyybQDHD_Q@mail.gmail.com> <7E40423E-7040-4AD5-9135-97032369CAC0@tycho.ncsc.mil> <CAK3OfOhfgfE65xrAsJy5iNLKuz8wNB8LikqHmiOYr5x8a7jmww@mail.gmail.com>
Date: Tue, 21 May 2013 14:18:02 -0400
In-Reply-To: <CAK3OfOhfgfE65xrAsJy5iNLKuz8wNB8LikqHmiOYr5x8a7jmww@mail.gmail.com> (Nico Williams's message of "Tue, 21 May 2013 12:21:54 -0500")
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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>>>>> "Nico" == Nico Williams <nico@cryptonector.com> writes:

    Nico> On Tue, May 21, 2013 at 11:18 AM, Kelley Burgin <kwburgi@tycho.ncsc.mil> wrote:
    >> Both Tom's and Nico's short-plaintext schemes miss something I'm
    >> looking for: the presence of the IV in the MAC
    >> computation. Otherwise the MAC value H is always the same for a
    >> given C (output of the encryption operation).

    Nico> When confounding the ciphertext of the confounder is included
    Nico> in MAC computation.  Why is this not sufficient?

The rest of the world (non-Kerberos) seems to use explicit IVs that are
sent in the clear just fine.  The only area I'd be concerned about is to
make sure an attacker does not gain an advantage if they know the
cipherstate between two messages.

it seems like using an explicit IV instead of a confounder is fairly
conservative cryptographic practice at this point.

From nico@cryptonector.com  Tue May 21 11:47:11 2013
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From: Nico Williams <nico@cryptonector.com>
To: Sam Hartman <hartmans-ietf@mit.edu>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Tue, May 21, 2013 at 1:18 PM, Sam Hartman <hartmans-ietf@mit.edu> wrote:
>     Nico> When confounding the ciphertext of the confounder is included
>     Nico> in MAC computation.  Why is this not sufficient?
>
> The rest of the world (non-Kerberos) seems to use explicit IVs that are
> sent in the clear just fine.  The only area I'd be concerned about is to
> make sure an attacker does not gain an advantage if they know the
> cipherstate between two messages.

That's not responsive.

> it seems like using an explicit IV instead of a confounder is fairly
> conservative cryptographic practice at this point.

But so is confounding.  Or, if confounding is not secure, maybe we
should find out.

Nico
--

From nico@cryptonector.com  Tue May 21 11:51:43 2013
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Date: Tue, 21 May 2013 13:51:30 -0500
Message-ID: <CAK3OfOgHbOxBUZDQbFYfX9hnLBMbioi4LZ9ccFEMU2A6Xn7cxw@mail.gmail.com>
From: Nico Williams <nico@cryptonector.com>
To: Kelley Burgin <kwburgi@tycho.ncsc.mil>
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Cc: kitten@ietf.org, Sam Hartman <hartmans-ietf@mit.edu>, Jeffrey Hutzelman <jhutz@cmu.edu>
Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Tue, May 21, 2013 at 12:05 PM, Kelley Burgin <kwburgi@tycho.ncsc.mil> wrote:
> In general, we want to
> 1. encrypt-then-mac,

Agreed.

> 2. include the IV directly in the MAC computation (so the MAC value H is
> different for the same output of the encryption operation C) and

Note that this is true with confounding anyways: every ciphertext of
the same plaintext (as provided by the application) is randomized
because the plaintext prepended with a nonce.

If there's something wrong with confounded encrypt-then-MAC (and
verify-then-decrypt) we should know, since we rely on confounding in
Kerberos today.

> 3. on the receiving end check the MAC before decryption (to save decrypting
> a long message only to find out later that the MAC doesn't verify).

And to avoid padding attacks.  (It helps to have no padding, of course.)

>
> I'm probably fine with a scheme that doesn't do the last two in
> short-plaintext cases (like Tom's and Nico's). However, to achieve all
> three, the nonce needs to be sent as part of the ciphertext.

No, my scheme gets you all three.  Confounding does not preclude any
of (1), (2), nor (3).

Nico
--

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From: Sam Hartman <hartmans-ietf@mit.edu>
To: Nico Williams <nico@cryptonector.com>
References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu> <22606_1369111554_r4L4jrrH023245_CAK3OfOiRsqC1RxbU96OGzOUj0=UEcQbXNKPrhBAgYyybQDHD_Q@mail.gmail.com> <1369154928.2711.772.camel@minbar.fac.cs.cmu.edu> <5F29C375-8261-41B2-B188-1938C6201ABD@tycho.ncsc.mil> <CAK3OfOgHbOxBUZDQbFYfX9hnLBMbioi4LZ9ccFEMU2A6Xn7cxw@mail.gmail.com>
Date: Tue, 21 May 2013 14:56:45 -0400
In-Reply-To: <CAK3OfOgHbOxBUZDQbFYfX9hnLBMbioi4LZ9ccFEMU2A6Xn7cxw@mail.gmail.com> (Nico Williams's message of "Tue, 21 May 2013 13:51:30 -0500")
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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>>>>> "Nico" == Nico Williams <nico@cryptonector.com> writes:

    Nico> Note that this is true with confounding anyways: every
    Nico> ciphertext of the same plaintext (as provided by the
    Nico> application) is randomized because the plaintext prepended
    Nico> with a nonce.

Note that having a nonce including in the IV also gets you this.  It's
quite important that two encryptions of the same plaintext result in
different ciphertexts.

From hotz@jpl.nasa.gov  Tue May 21 11:59:37 2013
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Subject: Re: [kitten] OT: ktutil and x-realm keys (Re: Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00)
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On May 20, 2013, at 5:04 PM, Nico Williams <nico@cryptonector.com> =
wrote:

> On Mon, May 20, 2013 at 6:46 PM, Henry B. Hotz <hotz@jpl.nasa.gov> =
wrote:
>> On May 16, 2013, at 9:36 AM, Greg Hudson <ghudson@MIT.EDU> wrote:
>>> * Cross-realm TGTs are currently managed by entering the same =
password
>>> at two KDCs to get the same keys.  If each KDC uses a random salt, =
they
>>> won't have the same keys.
>>=20
>> Obviously off-topic, but I've advocated for a "keytab import" =
administrative function as a way to avoid retyping passwords in this =
case.  Yeah, yeah, "write it yourself, it's open-source", I know.
>=20
> I don't think that's the best way to implement this.  As long as we
> must have password-based x-realm keys

But that's the point.  They shouldn't be password-based at all.  The =
string-to-key function isn't needed to make the tgs exchanges work.  All =
implementations can already generate random keys.  All implementations =
can already *export* keytab files independent of the password.  Just add =
the inverse operation.

See slide 16 of my 2007 AFS BP workshop presentation for how it works =
for Heimdal<->Heimdal cross-realm.  (I neglected to say you start with =
an "add -r" or two.)

> the way it should work is that
> one admin creates an x-realm princ on on realm, then the other realm's
> admin does an AS exchange to fetch the salt (and other s2kparams) and
> validate the password they've been told on the phone/whatever, then
> the key gets added to that realm.  This is, also, how password-based
> keys should be added to keytabs (to fetch the salt and other
> s2kparams).
>=20
> But this is off-topic, and also off-topic: we really need
> password-authenticated DH-exchanged x-realm keys and PKI-authenticated
> DH-exchanged x-realm keys.  I.e., PKCROSS.
>=20
> Nico
> --

------------------------------------------------------
The opinions expressed in this message are mine,
not those of Caltech, JPL, NASA, or the US Government.
Henry.B.Hotz@jpl.nasa.gov, or hbhotz@oxy.edu


From tlyu@mit.edu  Tue May 21 12:53:09 2013
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To: Kelley Burgin <kwburgi@tycho.ncsc.mil>
References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu> <CAK3OfOiRsqC1RxbU96OGzOUj0=UEcQbXNKPrhBAgYyybQDHD_Q@mail.gmail.com> <7E40423E-7040-4AD5-9135-97032369CAC0@tycho.ncsc.mil>
From: Tom Yu <tlyu@MIT.EDU>
Date: Tue, 21 May 2013 15:52:56 -0400
In-Reply-To: <7E40423E-7040-4AD5-9135-97032369CAC0@tycho.ncsc.mil> (Kelley Burgin's message of "Tue, 21 May 2013 12:18:55 -0400")
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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Kelley Burgin <kwburgi@tycho.ncsc.mil> writes:

> Both Tom's and Nico's short-plaintext schemes miss something I'm
> looking for: the presence of the IV in the MAC computation. Otherwise
> the MAC value H is always the same for a given C (output of the
> encryption operation).

I think both my proposal and Nico's use the nonce rather than the IV,
but they should have the same amount of entropy.  That should be
sufficient to prevent multiple encryptions of the same plaintext from
producing identical ciphertext.

> In general, we want to encrypt-then-mac, include the IV directly in
> the MAC computation and on the receiving end check the MAC before
> decryption (to save decrypting a long message only to find out later
> that the MAC doesn't verify). I'm probably fine with a scheme that
> doesn't do the last two in short-plaintext cases (like Tom's and
> Nico's). However, to achieve all three, the nonce needs to be sent as
> part of the ciphertext.
>
> Here are my comments on the two proposed short-plaintext schemes:
>
> In Tom's scheme for short-plaintext cases, it seems that duplicate
> information is being sent, if I understand correctly: isn't C1 a
> subset of the bits of N1? If so, it would be useful to include part of
> the IV in the MAC computation instead of C1 to diversify the MAC
> values for a given C.

I think I chose variable names poorly; they are not redundant.  C1 is
the the first plen bytes of the nonce N.  N1 is the single-block
output of Enc-CBC(Ke, plaintext | nullpad, IV) and does not contain
any plaintext bits of the nonce.

If the nonce N is random, it provides just as much randomization of
the ciphertext as the IV would (assuming they're independent of the
cipherstate).

> Tom's:
> [
> plen = len(plaintext)
> if plen < blocksize:
>  C = Enc-CBC(Ke, plaintext | nullpad, IV)
>  N1 = C[1..blocksize]
>  C1 = N[1..plen]
>  H = HMAC(Ki, N1 | C1)
>  ciphertext = N1 | C1 | H[1..h]
> ]
>
> could change to (note the receiver has to decrypt first to recover the
> IV, then verify the MAC)
>
> [
> plen = len(plaintext)
> if plen < blocksize:
>  C = Enc-CBC(Ke, plaintext | nullpad, IV)
>  IV* = IV[1..plen]     <-- don't truncate N1, use IV instead
> H = HMAC(Ki, C | IV*)
> ciphertext = C | IV* | H[1..h]
> ]

That's not too different from the following:

plen = len(plaintext)
if plen < blocksize:
  C = Enc-CBC(Ke, plaintext | nullpad, IV)
  N* = N[1..plen]
  H = HMAC(Ki, C | N*)
  ciphertext = C | N* | H[1..h]

It's mostly a question of whether you send the truncated IV directly
or whether you send the truncated nonce instead.

> Nico's could also be modified to include the IV in the MAC
> computation, without expanding the ciphertext:
>
> Nico's:
> [
>   C = E(Ke, N | plaintext, cipherstate)
>   H = HMAC(Ki, C)
>   ciphertext = C, H

Nico's version includes the nonce N, which the current document
specifies to be random.

> and corresponding change to the decrypt side:
>
>   (C, H) = ciphertext
>   if (H != HMAC(Ki, C)[1..h])
>      stop, report error
>   IV = cipherstate
>   (N, P) = D(Ke, C, IV)
>   cipherState = N
> ]
>
> could change to
>
> [
>   C = E(Ke, N | plaintext, cipherstate)
>   H = HMAC(Ki, N | C)   <-- added nonce here
>   ciphertext = C, H
>
> decrypt
>
>   (C, H) = ciphertext
>   IV = cipherstate   <-- decrypt first to recover the nonce, then
> check MAC
>   (N, P) = D(Ke, C, IV)
>   if (H != HMAC(Ki, N | C)[1..h])
>      stop, report error
>   cipherState = N
> ]
>
>
>
> On May 21, 2013, at 12:45 AM, Nico Williams wrote:
>
>> On Mon, May 20, 2013 at 10:58 PM, Tom Yu <tlyu@mit.edu> wrote:
>>> Nico Williams <nico@cryptonector.com> writes:
>>>> On Mon, May 20, 2013 at 7:21 PM, Tom Yu <tlyu@mit.edu> wrote:
>>>>> Nico Williams <nico@cryptonector.com> writes:
>>>>>> I don't see the problem.  In the short-plaintext case we'd have:
>>>>>>
>>>>>>   C = E(Ke, N | plaintext, cipherstate)
>>>>>>   H = HMAC(Ki, C)
>>>>>>   ciphertext = C
>>>>>
>>>>> That's not quite right, unless you're redefining E.  If E is
>>>>> SP800-38A+ "CBC-CS3", it doesn't really work unless
>>>>> len(plaintext) is
>>>>> greater than the blocksize.  We can still send a truncated nonce
>>>>> instead of a truncated IV, because we can recover the entire IV on
>>>>> decryption.
>>>>
>>>> Here E() operates on a plaintext 16-31 bytes long: E | P.  There's
>>>> no problem.
>>>
>>> I think you mean the plaintext is N | plaintext.  It sounds like
>>
>> That's what I wrote, yes :)
>>
>>> you're making the short-plaintext encryption change to using a
>>> confounder, which the current document seems to deliberately avoid.
>>
>> I don't know why the current document avoids confounding, not even
>> whether it does so deliberately or by accident -- the topic is not
>> addressed.  Section 1 addresses differences from aes-cts-hmac-sha-1,
>> but does not cover this one; it should.
>>
>> Nico
>> --

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Date: Tue, 21 May 2013 15:05:17 -0500
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From: Nico Williams <nico@cryptonector.com>
To: Sam Hartman <hartmans-ietf@mit.edu>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Tue, May 21, 2013 at 1:56 PM, Sam Hartman <hartmans-ietf@mit.edu> wrote:
>>>>>> "Nico" == Nico Williams <nico@cryptonector.com> writes:
>
>     Nico> Note that this is true with confounding anyways: every
>     Nico> ciphertext of the same plaintext (as provided by the
>     Nico> application) is randomized because the plaintext prepended
>     Nico> with a nonce.
>
> Note that having a nonce including in the IV also gets you this.  It's
> quite important that two encryptions of the same plaintext result in
> different ciphertexts.

There's no disagreement as to that.  I'm happy to not confound.  But
while you can tell me that not confounding is fine till your face
turns blue, that doesn't address the short plaintext issue.  Nor does
it address the need for some text explaining the departure from
Kerberos tradition -- I don't think strong justification is needed,
mind you, as I'm sold on it (at least for plaintexts 16 bytes or
longer).

Nico
--

From jhutz@cmu.edu  Tue May 21 13:40:08 2013
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Tue, 2013-05-21 at 14:18 -0400, Sam Hartman wrote:


> The rest of the world (non-Kerberos) seems to use explicit IVs that are
> sent in the clear just fine.  The only area I'd be concerned about is to
> make sure an attacker does not gain an advantage if they know the
> cipherstate between two messages.
> 
> it seems like using an explicit IV instead of a confounder is fairly
> conservative cryptographic practice at this point.

You seem to be replying to Nico with an attempt to answer my question,
or at least part of it.  When I said we should be conservative, I meant
that departures from existing designs should not be arbitrary or
gratuitous.  There needs to be a reason for the change, and there needs
to be some confidence that the change does not introduce a new problem.

I think we can agree that introducing an explicit IV does not create a
worse situation than the fixed IV used in existing enctypes.  And I
could come up with some reasons for doing so, but I'd rather hear the
actual reasons.

On the other hand, I am very nervous about omitting the random secret
confounder used by existing enctypes.  So far, I have seen neither an
indication of why this is necessary or why introducing a public IV makes
a secret confounder unnecessary.

-- Jeff


From tlyu@mit.edu  Tue May 21 13:45:39 2013
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To: Nico Williams <nico@cryptonector.com>
References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu> <CAK3OfOiRsqC1RxbU96OGzOUj0=UEcQbXNKPrhBAgYyybQDHD_Q@mail.gmail.com> <7E40423E-7040-4AD5-9135-97032369CAC0@tycho.ncsc.mil> <CAK3OfOhfgfE65xrAsJy5iNLKuz8wNB8LikqHmiOYr5x8a7jmww@mail.gmail.com> <tsl8v38urhh.fsf@mit.edu> <CAK3OfOh04vt8VXX3ynP7oyiYFXDQ_dmZ6=30qGEEAa5HvrNtTA@mail.gmail.com>
From: Tom Yu <tlyu@MIT.EDU>
Date: Tue, 21 May 2013 16:45:26 -0400
In-Reply-To: <CAK3OfOh04vt8VXX3ynP7oyiYFXDQ_dmZ6=30qGEEAa5HvrNtTA@mail.gmail.com> (Nico Williams's message of "Tue, 21 May 2013 13:45:44 -0500")
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Nico Williams <nico@cryptonector.com> writes:

>> it seems like using an explicit IV instead of a confounder is fairly
>> conservative cryptographic practice at this point.
>
> But so is confounding.  Or, if confounding is not secure, maybe we
> should find out.

I think CBC with explicit random IV is better analyzed in the
literature.  Encrypt-then-MAC is provably IND-CCA and INT-CTXT secure
given some reasonable assumptions about the MAC and the encryption
scheme.  (Bellare and Namprempre, "Authenticated Encryption: Relations
among notions and analysis of the generic composition paradigm",
2000.)

The "simplified profile" in RFC 3961 (prepend confounder, then
independently MAC and CBC-encrypt with zero IV) is provably IND-CCA
and INT-CTXT secure.  See Boldyreva and Kumar, "Provable-Security
Analysis of Authenticated Encryption in Kerberos", 2007.  Among other
things, it aruges that CBC encryption with zero IV and random
confounder is at least as secure as CBC encryption with random IV.

From tlyu@mit.edu  Tue May 21 15:13:33 2013
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To: Jeffrey Hutzelman <jhutz@cmu.edu>
References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu> <CAK3OfOiRsqC1RxbU96OGzOUj0=UEcQbXNKPrhBAgYyybQDHD_Q@mail.gmail.com> <7E40423E-7040-4AD5-9135-97032369CAC0@tycho.ncsc.mil> <CAK3OfOhfgfE65xrAsJy5iNLKuz8wNB8LikqHmiOYr5x8a7jmww@mail.gmail.com> <1223_1369160296_r4LIIFoA001408_tsl8v38urhh.fsf@mit.edu> <1369168798.2711.787.camel@minbar.fac.cs.cmu.edu>
From: Tom Yu <tlyu@MIT.EDU>
Date: Tue, 21 May 2013 18:13:21 -0400
In-Reply-To: <1369168798.2711.787.camel@minbar.fac.cs.cmu.edu> (Jeffrey Hutzelman's message of "Tue, 21 May 2013 16:39:58 -0400")
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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Jeffrey Hutzelman <jhutz@cmu.edu> writes:

> On the other hand, I am very nervous about omitting the random secret
> confounder used by existing enctypes.  So far, I have seen neither an
> indication of why this is necessary or why introducing a public IV makes
> a secret confounder unnecessary.

See the references I posted.  If a random confounder provides
additional security properties that a public IV does not, it would be
useful to know what they are.  It may be there's a nontrivial benefit
to having a random secret confounder, but I haven't found one yet.

From kwburgi@tycho.ncsc.mil  Wed May 22 08:36:04 2013
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From: Kelley Burgin <kwburgi@tycho.ncsc.mil>
To: Nico Williams <nico@cryptonector.com>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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Nico,

I had forgotten about the first block of cipher being the encryption  
of the IV - you're right that your scheme achieves all 3 security  
goals below. I haven't thought more about Tom's yet, but agree that we  
need to address the short-plaintext issue in the document and I'm  
happy to include whichever scheme we agree on.

The non-security related reasons (in response to you and Jeff) for the  
decisions made in my draft, which deviate from Kerberos tradition are:

The draft is intended to support the Suite B profile for Kerberos  
draft. Suite B is more than a set of algorithm choices - it provides  
NIST compliant security guidance and further systems requirements to  
achieve as secure a complete system as possible. There is no required  
"Suite B mode of encryption", but there is a rule that we follow: Use  
GCM when it makes sense, otherwise CBC (as specified in NIST  
SP800-38A, which specifies the use of padding and an explicit nonce).  
The krb-wg discussed using GCM years ago to conclude that it didn't  
make sense (counter rollover vulnerability issues), so we moved to CBC 
+padding+explicit IV. We eventually gave in to CTS mode around the  
same time the Addendum to SP800-38A came out standardizing CTS mode.

Moving to implicit IV would deviate from NIST standards (SP800-38A  
Section 6.2 specifies the IV be xored with the first block of  
plaintext and encrypted to output the first block of ciphertext). It  
would also break the Suite B mode rule. The other protocols (that  
we've written Suite B profiles for) where GCM doesn't make sense use  
CBC mode with explicit IV: IKEv2 (in IPSec RFC) and S/MIME.

There's also the performance issue that you pointed out that implicit  
IVs require an extra encryption and decryption operation per message,  
but send the same number of bytes on the wire as explicit IV, but this  
is less important to me than the Suite B/NIST philosophical issues  
above.

Kelley


On May 21, 2013, at 2:51 PM, Nico Williams wrote:

> On Tue, May 21, 2013 at 12:05 PM, Kelley Burgin <kwburgi@tycho.ncsc.mil 
> > wrote:
>> In general, we want to
>> 1. encrypt-then-mac,
>
> Agreed.
>
>> 2. include the IV directly in the MAC computation (so the MAC value  
>> H is
>> different for the same output of the encryption operation C) and
>
> Note that this is true with confounding anyways: every ciphertext of
> the same plaintext (as provided by the application) is randomized
> because the plaintext prepended with a nonce.
>
> If there's something wrong with confounded encrypt-then-MAC (and
> verify-then-decrypt) we should know, since we rely on confounding in
> Kerberos today.
>
>> 3. on the receiving end check the MAC before decryption (to save  
>> decrypting
>> a long message only to find out later that the MAC doesn't verify).
>
> And to avoid padding attacks.  (It helps to have no padding, of  
> course.)
>
>>
>> I'm probably fine with a scheme that doesn't do the last two in
>> short-plaintext cases (like Tom's and Nico's). However, to achieve  
>> all
>> three, the nonce needs to be sent as part of the ciphertext.
>
> No, my scheme gets you all three.  Confounding does not preclude any
> of (1), (2), nor (3).
>
> Nico
> --


From nico@cryptonector.com  Wed May 22 08:38:50 2013
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Date: Wed, 22 May 2013 10:38:38 -0500
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From: Nico Williams <nico@cryptonector.com>
To: Tom Yu <tlyu@mit.edu>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Tue, May 21, 2013 at 3:45 PM, Tom Yu <tlyu@mit.edu> wrote:
> I think CBC with explicit random IV is better analyzed in the
> literature.  Encrypt-then-MAC is provably IND-CCA and INT-CTXT secure
> given some reasonable assumptions about the MAC and the encryption
> scheme.  (Bellare and Namprempre, "Authenticated Encryption: Relations
> among notions and analysis of the generic composition paradigm",
> 2000.)
>
> The "simplified profile" in RFC 3961 (prepend confounder, then
> independently MAC and CBC-encrypt with zero IV) is provably IND-CCA
> and INT-CTXT secure.  See Boldyreva and Kumar, "Provable-Security
> Analysis of Authenticated Encryption in Kerberos", 2007.  Among other
> things, it aruges that CBC encryption with zero IV and random
> confounder is at least as secure as CBC encryption with random IV.

It should be obvious that confounding CBC (or CTS, which is a
variation on CBC) is at least as secure as CBC (or CTS) with random
IV.  It follows from the fact that encryption with CBC and a
confounder is the same as encrypting a random nonce (same size as an
IV) to get an IV for use in encrypting the original plaintext --
encrypting the nonce can't degrade security.

It is less obvious that confounding doesn't add security (and I think
it doesn't).  But then, CBC with a random IV meets our security needs
and there's plenty of analysis to back this up.

The main benefit to not confounding is performance: there's one fewer
encryption/decryption operation per-RFC3962 encryption/decryption
operation.  For small messages this is a big deal.

Some text for the intro section would be nice.  And a solution to the
short plaintext problem is critical (if nothing else because GSS
consumers are free to use shorter plaintexts and we don't know if they
do or don't; ditto AFS and other non-Internet protocols).  I'm happy
with either a counter or confounded short plaintext encryption
solution, and I'd prefer the counter one on account of performance
(again).

Nico
-- 

Nico
--

From nico@cryptonector.com  Wed May 22 08:51:53 2013
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From: Nico Williams <nico@cryptonector.com>
To: Kelley Burgin <kwburgi@tycho.ncsc.mil>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Wed, May 22, 2013 at 10:39 AM, Kelley Burgin <kwburgi@tycho.ncsc.mil> wrote:

Thanks.  This is what I was looking for.

I don't think confounding clashes philosophically with the NIST Suite
B requirements.  It clearly functions as CBC w/ random IV...  it uses
encryption to derive the IV from a nonce, but so what?  The
philosophical difference between CBC w/ random IV and CBC with
confounding seems about as strong as that between CBC and CTS.

That said: I'm happy to not confound, and I would found my personal
choice to dump confounding on the performance gain to be had from not
confounding.

As for short-plaintext, I think I prefer Tom's counter mode solution
(again, for performance reasons).

Nico
--

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To: Nico Williams <nico@cryptonector.com>
References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu> <CAK3OfOiRsqC1RxbU96OGzOUj0=UEcQbXNKPrhBAgYyybQDHD_Q@mail.gmail.com> <7E40423E-7040-4AD5-9135-97032369CAC0@tycho.ncsc.mil> <CAK3OfOhfgfE65xrAsJy5iNLKuz8wNB8LikqHmiOYr5x8a7jmww@mail.gmail.com> <tsl8v38urhh.fsf@mit.edu> <CAK3OfOh04vt8VXX3ynP7oyiYFXDQ_dmZ6=30qGEEAa5HvrNtTA@mail.gmail.com> <ldvtxlw83kp.fsf@cathode-dark-space.mit.edu> <CAK3OfOg7xFPop-XicoL4CzKN1rogH8XfgTqRnzb6aaAnX4AbOA@mail.gmail.com>
From: Tom Yu <tlyu@MIT.EDU>
Date: Wed, 22 May 2013 14:03:39 -0400
In-Reply-To: <CAK3OfOg7xFPop-XicoL4CzKN1rogH8XfgTqRnzb6aaAnX4AbOA@mail.gmail.com> (Nico Williams's message of "Wed, 22 May 2013 10:38:38 -0500")
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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Nico Williams <nico@cryptonector.com> writes:

> It should be obvious that confounding CBC (or CTS, which is a
> variation on CBC) is at least as secure as CBC (or CTS) with random
> IV.  It follows from the fact that encryption with CBC and a
> confounder is the same as encrypting a random nonce (same size as an
> IV) to get an IV for use in encrypting the original plaintext --
> encrypting the nonce can't degrade security.
>
> It is less obvious that confounding doesn't add security (and I think
> it doesn't).  But then, CBC with a random IV meets our security needs
> and there's plenty of analysis to back this up.

I think I generally agree with the above.  I'm not aware of any
significant specific benefit that a secret confounder provides beyond
what a public random IV does.  Anyone know of relevant results in the
research literature?

> The main benefit to not confounding is performance: there's one fewer
> encryption/decryption operation per-RFC3962 encryption/decryption
> operation.  For small messages this is a big deal.

CTS encryption and decryption aren't symmetric in cost.  CTS
encryption of a message can use an underlying CBC encryption primitive
and only need to invoke it once.  CTS decryption, on the other hand,
will need to invoke the underlying CBC decryption primitive twice in
the general case.  (It's possible to reduce it to only one invocation,
but not without making some questionable assumptions about the
internals of the CBC decryption primitive.)

> Some text for the intro section would be nice.  And a solution to the
> short plaintext problem is critical (if nothing else because GSS
> consumers are free to use shorter plaintexts and we don't know if they
> do or don't; ditto AFS and other non-Internet protocols).  I'm happy
> with either a counter or confounded short plaintext encryption
> solution, and I'd prefer the counter one on account of performance
> (again).

I agree that some additional text in the introduction explaining the
design choices would be useful.

From kwburgi@tycho.ncsc.mil  Wed May 22 12:05:57 2013
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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I'm happy to give an explanation of design choices in the document.  
(especially those that differ from Kerberos tradition)

Looking over Tom's short-plaintext scheme again, I see the mistake I  
made in reading the variables. It looks good to me, with one question:  
is len(C) ever anything but blocksize?

plen = len(plaintext)
if plen < blocksize:
  C = Enc-CBC(Ke, plaintext | nullpad, IV)
  N1 = C[1..blocksize]    <-- question here
  C1 = N[1..plen]
  H = HMAC(Ki, N1 | C1)
  ciphertext = N1 | C1 | H[1..h]

What is the feeling about including some text on the structure of  
salts (in particular the inclusion of random valid UTF-8 sequences) in  
the document? Does this make sense here? Is it worth a separate  
document?

Kelley

On May 22, 2013, at 2:03 PM, Tom Yu wrote:

> Nico Williams <nico@cryptonector.com> writes:
>
>> It should be obvious that confounding CBC (or CTS, which is a
>> variation on CBC) is at least as secure as CBC (or CTS) with random
>> IV.  It follows from the fact that encryption with CBC and a
>> confounder is the same as encrypting a random nonce (same size as an
>> IV) to get an IV for use in encrypting the original plaintext --
>> encrypting the nonce can't degrade security.
>>
>> It is less obvious that confounding doesn't add security (and I think
>> it doesn't).  But then, CBC with a random IV meets our security needs
>> and there's plenty of analysis to back this up.
>
> I think I generally agree with the above.  I'm not aware of any
> significant specific benefit that a secret confounder provides beyond
> what a public random IV does.  Anyone know of relevant results in the
> research literature?
>
>> The main benefit to not confounding is performance: there's one fewer
>> encryption/decryption operation per-RFC3962 encryption/decryption
>> operation.  For small messages this is a big deal.
>
> CTS encryption and decryption aren't symmetric in cost.  CTS
> encryption of a message can use an underlying CBC encryption primitive
> and only need to invoke it once.  CTS decryption, on the other hand,
> will need to invoke the underlying CBC decryption primitive twice in
> the general case.  (It's possible to reduce it to only one invocation,
> but not without making some questionable assumptions about the
> internals of the CBC decryption primitive.)
>
>> Some text for the intro section would be nice.  And a solution to the
>> short plaintext problem is critical (if nothing else because GSS
>> consumers are free to use shorter plaintexts and we don't know if  
>> they
>> do or don't; ditto AFS and other non-Internet protocols).  I'm happy
>> with either a counter or confounded short plaintext encryption
>> solution, and I'd prefer the counter one on account of performance
>> (again).
>
> I agree that some additional text in the introduction explaining the
> design choices would be useful.


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From: mrex@sap.com (Martin Rex)
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Cc: kitten@ietf.org, Sam Hartman <hartmans-ietf@mit.edu>, Jeffrey Hutzelman <jhutz@cmu.edu>
Subject: [kitten] Origins of the CBC padding scheme (PEM rather than PKCS#5?)
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Slightly off-topic:

Kelley Burgin wrote:
> 
> (the intended applications there don't have a problem with PKCS#5 padding)

I'm confused, where does the term "PKCS#5 padding" come from?

While there is a specific DES-CBC (and DES-EDE3-CBC) padding for
64-bit block ciphers described in PKCS#5 (e.g. v2.0 rfc2898),

  - that padding is strictly limited to 64-bit

  - that padding is explicitly described as
    "being taken from rfc1423" (->Privacy Enhanced Mail (PEM))

    http://tools.ietf.org/html/rfc2898#page-13


Curiously, rfc1423 is similarily limited to 64-bit block ciphers (DES):

    http://tools.ietf.org/html/rfc1423#page-3


A "generalization" of that padding scheme for block sizes up to 255 octets
can be found in PKCS#7 v1.5 end of section 10.3 (rfc2315):

  http://tools.ietf.org/html/rfc2315#page-22
    

        2.   Some content-encryption algorithms assume the
             input length is a multiple of k octets, where k > 1, and
             let the application define a method for handling inputs
             whose lengths are not a multiple of k octets. For such
             algorithms, the method shall be to pad the input at the
             trailing end with k - (l mod k) octets all having value k -
             (l mod k), where l is the length of the input. In other
             words, the input is padded at the trailing end with one of
             the following strings:

                      01 -- if l mod k = k-1
                     02 02 -- if l mod k = k-2
                                 .
                                 .
                                 .
                   k k ... k k -- if l mod k = 0

             The padding can be removed unambiguously since all input is
             padded and no padding string is a suffix of another. This
             padding method is well-defined if and only if k < 256;
             methods for larger k are an open issue for further study.


-Martin

From kwburgi@tycho.ncsc.mil  Thu May 23 05:46:00 2013
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Subject: Re: [kitten] Origins of the CBC padding scheme (PEM rather than PKCS#5?)
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Sorry for the confusion. I was referring to Section B.2.5 of PKCS#5  
v2.1 (AES-CBC-Pad) which points to RFC 5652 (CMS, derived from PKCS#7).

Kelley

On May 22, 2013, at 10:57 PM, Martin Rex wrote:

> Slightly off-topic:
>
> Kelley Burgin wrote:
>>
>> (the intended applications there don't have a problem with PKCS#5  
>> padding)
>
> I'm confused, where does the term "PKCS#5 padding" come from?
>
> While there is a specific DES-CBC (and DES-EDE3-CBC) padding for
> 64-bit block ciphers described in PKCS#5 (e.g. v2.0 rfc2898),
>
>  - that padding is strictly limited to 64-bit
>
>  - that padding is explicitly described as
>    "being taken from rfc1423" (->Privacy Enhanced Mail (PEM))
>
>    http://tools.ietf.org/html/rfc2898#page-13
>
>
> Curiously, rfc1423 is similarily limited to 64-bit block ciphers  
> (DES):
>
>    http://tools.ietf.org/html/rfc1423#page-3
>
>
> A "generalization" of that padding scheme for block sizes up to 255  
> octets
> can be found in PKCS#7 v1.5 end of section 10.3 (rfc2315):
>
>  http://tools.ietf.org/html/rfc2315#page-22
>
>
>        2.   Some content-encryption algorithms assume the
>             input length is a multiple of k octets, where k > 1, and
>             let the application define a method for handling inputs
>             whose lengths are not a multiple of k octets. For such
>             algorithms, the method shall be to pad the input at the
>             trailing end with k - (l mod k) octets all having value  
> k -
>             (l mod k), where l is the length of the input. In other
>             words, the input is padded at the trailing end with one of
>             the following strings:
>
>                      01 -- if l mod k = k-1
>                     02 02 -- if l mod k = k-2
>                                 .
>                                 .
>                                 .
>                   k k ... k k -- if l mod k = 0
>
>             The padding can be removed unambiguously since all input  
> is
>             padded and no padding string is a suffix of another. This
>             padding method is well-defined if and only if k < 256;
>             methods for larger k are an open issue for further study.
>
>
> -Martin


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From: Benjamin Kaduk <kaduk@MIT.EDU>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Wed, 22 May 2013, Kelley Burgin wrote:

> I'm happy to give an explanation of design choices in the document. 
> (especially those that differ from Kerberos tradition)

That would be good, thanks.

> What is the feeling about including some text on the structure of salts (in 
> particular the inclusion of random valid UTF-8 sequences) in the document? 
> Does this make sense here? Is it worth a separate document?

I think it would be reasonable to include a "suite B considerations" (or 
similar) section at the end, possibly even in the security considerations, 
noting that this enctype is proposed to support a suite B profile, which 
will want random salts, and that salts must be valid UTF-8.  Hmm, I wonder 
whether the concept of a "random valid UTF-8 sequence" is well-defined...

-Ben

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On Thu, May 23, 2013 at 10:05 AM, Benjamin Kaduk <kaduk@mit.edu> wrote:
> I think it would be reasonable to include a "suite B considerations" (or
> similar) section at the end, possibly even in the security considerations,
> noting that this enctype is proposed to support a suite B profile, which
> will want random salts, and that salts must be valid UTF-8.  Hmm, I wonder
> whether the concept of a "random valid UTF-8 sequence" is well-defined...

Zalgo comes to mind...

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From: Sam Hartman <hartmans-ietf@mit.edu>
To: Kelley Burgin <kwburgi@tycho.ncsc.mil>
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Date: Thu, 23 May 2013 15:19:24 -0400
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Subject: [kitten] Salts in aes sha2 draft
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Speaking as an individual.  Comments on the salt issue.


I think that thinking about salting and password hashing has advanced
significantly since 4120.

I think that including a section in a document defining a new enctype
updating our thinking on salting and password hashing would be valuable.

If I were wwriting that section I'd include:

1) value of random salts

2) Issues you run into with Kerberos

2.1) Specifically including the issue of finding salt to construct a
keytab

2.2) And cross-realm keys

3) Discuss mitigations for 2

3.1) How well does performing an as-req and looking at the etype-info2
work in both cases.  Probably fine for servers and perhaps not so fine
for cross-realm

3.2) Well, there is Nico's set/change password draft, that unfortunately
no one is interested in implementing.

From nico@cryptonector.com  Thu May 23 13:20:03 2013
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From: Nico Williams <nico@cryptonector.com>
To: Sam Hartman <hartmans-ietf@mit.edu>
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Subject: Re: [kitten] Salts in aes sha2 draft
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On Thu, May 23, 2013 at 2:19 PM, Sam Hartman <hartmans-ietf@mit.edu> wrote:
> 1) value of random salts

If random salts are valuable (I think they are, though *any* salt
that's different for each principal gets us most of the value of
salts) then salts must be changed when passwords are changed.
Otherwise the fact that a salt was initially selected randomly loses
the benefit of having been selected randomly: an attacker can see what
the salt is, after all.

> 2) Issues you run into with Kerberos
>
> 2.1) Specifically including the issue of finding salt to construct a
> keytab
>
> 2.2) And cross-realm keys

They are both exactly the same issue.  In both cases the resulting
keys are added to a sort of key database.

> 3) Discuss mitigations for 2

The only mitigations are: a) send an AS-REQ to learn the salt (and
other s2kparams) with, or b) have the salt (and other s2kparams) at
hand for off-line key generation.

> 3.1) How well does performing an as-req and looking at the etype-info2
> work in both cases.  Probably fine for servers and perhaps not so fine
> for cross-realm

It should work for both cases.  A cross-realm relationship might be
uni-directional, and there might be a firewall in place preventing
AS-REQs in one direction, therefore the key should be added first to
the realm whose KDCs are reachable by the other realm's admins.

> 3.2) Well, there is Nico's set/change password draft, that unfortunately
> no one is interested in implementing.

Right.  Forget it.  Well, now that more implementations have/use ASN.1
compilers it might be worth reviving, but then, I think I'd just as
well do a JSON-based change/set password protocol.

Nico
--

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From: Sam Hartman <hartmans-ietf@mit.edu>
To: Nico Williams <nico@cryptonector.com>
References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu> <CAK3OfOiRsqC1RxbU96OGzOUj0=UEcQbXNKPrhBAgYyybQDHD_Q@mail.gmail.com> <7E40423E-7040-4AD5-9135-97032369CAC0@tycho.ncsc.mil> <CAK3OfOhfgfE65xrAsJy5iNLKuz8wNB8LikqHmiOYr5x8a7jmww@mail.gmail.com> <tsl8v38urhh.fsf@mit.edu> <CAK3OfOh04vt8VXX3ynP7oyiYFXDQ_dmZ6=30qGEEAa5HvrNtTA@mail.gmail.com> <ldvtxlw83kp.fsf@cathode-dark-space.mit.edu> <CAK3OfOg7xFPop-XicoL4CzKN1rogH8XfgTqRnzb6aaAnX4AbOA@mail.gmail.com> <ldvy5b66gec.fsf@cathode-dark-space.mit.edu> <8138C036-FAA0-43E1-A952-902FE998A640@tycho.ncsc.mil> <tsltxltjygz.fsf_-_@mit.edu> <CAK3OfOjx1==8g+6pL8V5sBcDo2S+t+o30XwcgYW-jiDf0-1y1A@mail.gmail.com>
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In-Reply-To: <CAK3OfOjx1==8g+6pL8V5sBcDo2S+t+o30XwcgYW-jiDf0-1y1A@mail.gmail.com> (Nico Williams's message of "Thu, 23 May 2013 14:39:37 -0500")
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Subject: Re: [kitten] Salts in aes sha2 draft
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>>>>> "Nico" == Nico Williams <nico@cryptonector.com> writes:

    Nico> They are both exactly the same issue.  In both cases the
    Nico> resulting keys are added to a sort of key database.

I don't think they are exactly the same.  I can think of many fewer
reasons a realm would permit an AS-req with a cross-realm princ as a
client than it would for a server.

From nico@cryptonector.com  Thu May 23 14:16:20 2013
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Date: Thu, 23 May 2013 15:32:41 -0500
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From: Nico Williams <nico@cryptonector.com>
To: Sam Hartman <hartmans-ietf@mit.edu>
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Cc: kitten@ietf.org, Jeffrey Hutzelman <jhutz@cmu.edu>
Subject: Re: [kitten] Salts in aes sha2 draft
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On Thu, May 23, 2013 at 3:12 PM, Sam Hartman <hartmans-ietf@mit.edu> wrote:
>>>>>> "Nico" == Nico Williams <nico@cryptonector.com> writes:
>
>     Nico> They are both exactly the same issue.  In both cases the
>     Nico> resulting keys are added to a sort of key database.
>
> I don't think they are exactly the same.  I can think of many fewer
> reasons a realm would permit an AS-req with a cross-realm princ as a
> client than it would for a server.

True, but though it might not permit it it should still serve the
etype info2, so we get the salt for this purpose.

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From: Nico Williams <nico@cryptonector.com>
To: Sam Hartman <hartmans-ietf@mit.edu>
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Subject: Re: [kitten] Salts in aes sha2 draft
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Alternative mitigation for x-realm: don't randomize the salt.  The
x-realm password had better be very strong anyways.

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Subject: Re: [kitten] Salts in aes sha2 draft
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On Thu, 23 May 2013, Sam Hartman wrote:

>>>>>> "Nico" == Nico Williams <nico@cryptonector.com> writes:
>
> I don't think they are exactly the same.  I can think of many fewer
> reasons a realm would permit an AS-req with a cross-realm princ as a
> client than it would for a server.

Didn't we talk about this (elsewhere) when considering how to unilaterally 
rekey a cross-realm trust?  The AS protocol only had one realm field, was 
my recollection, so a cross-realm AS-req is impossible.

-Ben

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References: <mailman.51.1368644424.24718.kitten@ietf.org> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu> <CAK3OfOiRsqC1RxbU96OGzOUj0=UEcQbXNKPrhBAgYyybQDHD_Q@mail.gmail.com> <7E40423E-7040-4AD5-9135-97032369CAC0@tycho.ncsc.mil> <CAK3OfOhfgfE65xrAsJy5iNLKuz8wNB8LikqHmiOYr5x8a7jmww@mail.gmail.com> <tsl8v38urhh.fsf@mit.edu> <CAK3OfOh04vt8VXX3ynP7oyiYFXDQ_dmZ6=30qGEEAa5HvrNtTA@mail.gmail.com> <ldvtxlw83kp.fsf@cathode-dark-space.mit.edu> <CAK3OfOg7xFPop-XicoL4CzKN1rogH8XfgTqRnzb6aaAnX4AbOA@mail.gmail.com> <ldvy5b66gec.fsf@cathode-dark-space.mit.edu> <8138C036-FAA0-43E1-A952-902FE998A640@tycho.ncsc.mil> <tsltxltjygz.fsf_-_@mit.edu> <CAK3OfOjx1==8g+6pL8V5sBcDo2S+t+o30XwcgYW-jiDf0-1y1A@mail.gmail.com> <tslhahtjw00.fsf@mit.edu> <29927_1369345603_r4NLkgCg030787_alpine.GSO.1.10.1305231657190.9389@multics.mit.edu>
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Cc: kitten@ietf.org, Sam Hartman <hartmans-ietf@MIT.EDU>, jhutz@cmu.edu
Subject: Re: [kitten] Salts in aes sha2 draft
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On Thu, 2013-05-23 at 16:59 -0400, Benjamin Kaduk wrote:
> On Thu, 23 May 2013, Sam Hartman wrote:
> 
> >>>>>> "Nico" == Nico Williams <nico@cryptonector.com> writes:
> >
> > I don't think they are exactly the same.  I can think of many fewer
> > reasons a realm would permit an AS-req with a cross-realm princ as a
> > client than it would for a server.
> 
> Didn't we talk about this (elsewhere) when considering how to unilaterally 
> rekey a cross-realm trust?  The AS protocol only had one realm field, was 
> my recollection, so a cross-realm AS-req is impossible.

Right; there's no way to express an AS-REQ in which the client and
service are not in the same realm.


From nico@cryptonector.com  Thu May 23 17:16:55 2013
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References: <mailman.51.1368644424.24718.kitten@ietf.org> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu> <CAK3OfOiRsqC1RxbU96OGzOUj0=UEcQbXNKPrhBAgYyybQDHD_Q@mail.gmail.com> <7E40423E-7040-4AD5-9135-97032369CAC0@tycho.ncsc.mil> <CAK3OfOhfgfE65xrAsJy5iNLKuz8wNB8LikqHmiOYr5x8a7jmww@mail.gmail.com> <tsl8v38urhh.fsf@mit.edu> <CAK3OfOh04vt8VXX3ynP7oyiYFXDQ_dmZ6=30qGEEAa5HvrNtTA@mail.gmail.com> <ldvtxlw83kp.fsf@cathode-dark-space.mit.edu> <CAK3OfOg7xFPop-XicoL4CzKN1rogH8XfgTqRnzb6aaAnX4AbOA@mail.gmail.com> <ldvy5b66gec.fsf@cathode-dark-space.mit.edu> <8138C036-FAA0-43E1-A952-902FE998A640@tycho.ncsc.mil> <tsltxltjygz.fsf_-_@mit.edu> <CAK3OfOjx1==8g+6pL8V5sBcDo2S+t+o30XwcgYW-jiDf0-1y1A@mail.gmail.com> <tslhahtjw00.fsf@mit.edu> <29927_1369345603_r4NLkgCg030787_alpine.GSO.1.10.1305231657190.9389@multics.mit.edu> <1369352483.2915.33.camel@destiny.pc.cs.cmu.edu>
Date: Thu, 23 May 2013 19:16:18 -0500
Message-ID: <CAK3OfOiqfiQADi0h6y4JgVUYS920vQu7R8PrzWurdonSM6ao5w@mail.gmail.com>
From: Nico Williams <nico@cryptonector.com>
To: Jeffrey Hutzelman <jhutz@cmu.edu>
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Cc: kitten@ietf.org, Sam Hartman <hartmans-ietf@mit.edu>
Subject: Re: [kitten] Salts in aes sha2 draft
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On Thu, May 23, 2013 at 6:41 PM, Jeffrey Hutzelman <jhutz@cmu.edu> wrote:
> On Thu, 2013-05-23 at 16:59 -0400, Benjamin Kaduk wrote:
>> On Thu, 23 May 2013, Sam Hartman wrote:
>>
>> >>>>>> "Nico" == Nico Williams <nico@cryptonector.com> writes:
>> >
>> > I don't think they are exactly the same.  I can think of many fewer
>> > reasons a realm would permit an AS-req with a cross-realm princ as a
>> > client than it would for a server.
>>
>> Didn't we talk about this (elsewhere) when considering how to unilaterally
>> rekey a cross-realm trust?  The AS protocol only had one realm field, was
>> my recollection, so a cross-realm AS-req is impossible.
>
> Right; there's no way to express an AS-REQ in which the client and
> service are not in the same realm.

Right, but here the client principal *is* the x-realm principal in
question, the service principal is irrelevant (could be the same as
the client principal) and the KDC can be in either realm (whichever
one the client principal was created in).  Of course, if the x-realm
principal is created first in the KDB of the *other* realm then
there's no other principals that could be used as the service
principal but itself.  Either way, it should work.  Ah, and completing
the AS exchange has some value, particularly if the service is the
same as the client principal: to validate the key.

Keeping the salt secret (and if it's randomly generated) adds to the
strength of... what should be a strong key to begin with, so I don't
see any point in disallowing the AS exchange in this case.  But it
could be disabled after the key is exchanged.

Anyways, we really need a DH x-realm key exchange protocol.  And
better: PKCROSS (and we don't need Ticket extensions, just encrypted
(or authenticated anyways) PA-DATA.

Nico
--

From hartmans@mit.edu  Thu May 23 19:23:27 2013
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From: Sam Hartman <hartmans-ietf@mit.edu>
To: Nico Williams <nico@cryptonector.com>
References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu> <CAK3OfOiRsqC1RxbU96OGzOUj0=UEcQbXNKPrhBAgYyybQDHD_Q@mail.gmail.com> <7E40423E-7040-4AD5-9135-97032369CAC0@tycho.ncsc.mil> <CAK3OfOhfgfE65xrAsJy5iNLKuz8wNB8LikqHmiOYr5x8a7jmww@mail.gmail.com> <tsl8v38urhh.fsf@mit.edu> <CAK3OfOh04vt8VXX3ynP7oyiYFXDQ_dmZ6=30qGEEAa5HvrNtTA@mail.gmail.com> <ldvtxlw83kp.fsf@cathode-dark-space.mit.edu> <CAK3OfOg7xFPop-XicoL4CzKN1rogH8XfgTqRnzb6aaAnX4AbOA@mail.gmail.com> <ldvy5b66gec.fsf@cathode-dark-space.mit.edu> <8138C036-FAA0-43E1-A952-902FE998A640@tycho.ncsc.mil> <tsltxltjygz.fsf_-_@mit.edu> <CAK3OfOjx1==8g+6pL8V5sBcDo2S+t+o30XwcgYW-jiDf0-1y1A@mail.gmail.com> <tslhahtjw00.fsf@mit.edu> <CAK3OfOghdirdoDdWOhpXJ1oMD3yZrcaOFM_k1b+1Z7cSouf0vQ@mail.gmail.com>
Date: Thu, 23 May 2013 22:23:18 -0400
In-Reply-To: <CAK3OfOghdirdoDdWOhpXJ1oMD3yZrcaOFM_k1b+1Z7cSouf0vQ@mail.gmail.com> (Nico Williams's message of "Thu, 23 May 2013 15:32:41 -0500")
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Cc: kitten@ietf.org, Sam Hartman <hartmans-ietf@mit.edu>, Jeffrey Hutzelman <jhutz@cmu.edu>
Subject: Re: [kitten] Salts in aes sha2 draft
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>>>>> "Nico" == Nico Williams <nico@cryptonector.com> writes:

    Nico> On Thu, May 23, 2013 at 3:12 PM, Sam Hartman <hartmans-ietf@mit.edu> wrote:
    >>>>>>> "Nico" == Nico Williams <nico@cryptonector.com> writes:
    >> 
    Nico> They are both exactly the same issue.  In both cases the
    Nico> resulting keys are added to a sort of key database.
    >> 
    >> I don't think they are exactly the same.  I can think of many
    >> fewer reasons a realm would permit an AS-req with a cross-realm
    >> princ as a client than it would for a server.

    Nico> True, but though it might not permit it it should still serve
    Nico> the etype info2, so we get the salt for this purpose.

Treating the issues differently so we could consider whether we want to
recommend stuff like this was my primary motivation for calling out
xrealm separately.


From tlyu@mit.edu  Thu May 23 20:05:44 2013
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To: Nico Williams <nico@cryptonector.com>
References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu> <CAK3OfOiRsqC1RxbU96OGzOUj0=UEcQbXNKPrhBAgYyybQDHD_Q@mail.gmail.com> <7E40423E-7040-4AD5-9135-97032369CAC0@tycho.ncsc.mil> <CAK3OfOhfgfE65xrAsJy5iNLKuz8wNB8LikqHmiOYr5x8a7jmww@mail.gmail.com> <tsl8v38urhh.fsf@mit.edu> <CAK3OfOh04vt8VXX3ynP7oyiYFXDQ_dmZ6=30qGEEAa5HvrNtTA@mail.gmail.com> <ldvtxlw83kp.fsf@cathode-dark-space.mit.edu> <CAK3OfOg7xFPop-XicoL4CzKN1rogH8XfgTqRnzb6aaAnX4AbOA@mail.gmail.com>
From: Tom Yu <tlyu@MIT.EDU>
Date: Thu, 23 May 2013 23:05:30 -0400
In-Reply-To: <CAK3OfOg7xFPop-XicoL4CzKN1rogH8XfgTqRnzb6aaAnX4AbOA@mail.gmail.com> (Nico Williams's message of "Wed, 22 May 2013 10:38:38 -0500")
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Cc: kitten@ietf.org, Sam Hartman <hartmans-ietf@mit.edu>
Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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Nico Williams <nico@cryptonector.com> writes:

> Some text for the intro section would be nice.  And a solution to the
> short plaintext problem is critical (if nothing else because GSS
> consumers are free to use shorter plaintexts and we don't know if they
> do or don't; ditto AFS and other non-Internet protocols).  I'm happy
> with either a counter or confounded short plaintext encryption
> solution, and I'd prefer the counter one on account of performance
> (again).

As an implementor, I'm reluctant to use any scheme where the
short-plaintext case requires a substantially difference code path.
Such special cases increase the risk of bugs and interop problems.
I'm not sure it's better to reconsider PKCS#7-padded CBC mode with
random public IV or confounded CTS mode.

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From: Sam Hartman <hartmans-ietf@mit.edu>
To: Tom Yu <tlyu@MIT.EDU>
References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu> <CAK3OfOiRsqC1RxbU96OGzOUj0=UEcQbXNKPrhBAgYyybQDHD_Q@mail.gmail.com> <7E40423E-7040-4AD5-9135-97032369CAC0@tycho.ncsc.mil> <CAK3OfOhfgfE65xrAsJy5iNLKuz8wNB8LikqHmiOYr5x8a7jmww@mail.gmail.com> <tsl8v38urhh.fsf@mit.edu> <CAK3OfOh04vt8VXX3ynP7oyiYFXDQ_dmZ6=30qGEEAa5HvrNtTA@mail.gmail.com> <ldvtxlw83kp.fsf@cathode-dark-space.mit.edu> <CAK3OfOg7xFPop-XicoL4CzKN1rogH8XfgTqRnzb6aaAnX4AbOA@mail.gmail.com> <ldvr4gx9ix1.fsf@cathode-dark-space.mit.edu>
Date: Thu, 23 May 2013 23:20:31 -0400
In-Reply-To: <ldvr4gx9ix1.fsf@cathode-dark-space.mit.edu> (Tom Yu's message of "Thu, 23 May 2013 23:05:30 -0400")
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Cc: kitten@ietf.org, Sam Hartman <hartmans-ietf@mit.edu>
Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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>>>>> "Tom" == Tom Yu <tlyu@MIT.EDU> writes:

    Tom> Nico Williams <nico@cryptonector.com> writes:
    >> Some text for the intro section would be nice.  And a solution to
    >> the short plaintext problem is critical (if nothing else because
    >> GSS consumers are free to use shorter plaintexts and we don't
    >> know if they do or don't; ditto AFS and other non-Internet
    >> protocols).  I'm happy with either a counter or confounded short
    >> plaintext encryption solution, and I'd prefer the counter one on
    >> account of performance (again).

I'd like to better understand how GSS consumers contribute to the
short-plaintext problem.  won't the CFX header always be large enough to
get us a block?

From nico@cryptonector.com  Thu May 23 22:30:15 2013
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Date: Fri, 24 May 2013 00:30:02 -0500
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From: Nico Williams <nico@cryptonector.com>
To: Sam Hartman <hartmans-ietf@mit.edu>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Thu, May 23, 2013 at 10:20 PM, Sam Hartman <hartmans-ietf@mit.edu> wrote:
> I'd like to better understand how GSS consumers contribute to the
> short-plaintext problem.  won't the CFX header always be large enough to
> get us a block?

Oh, indeed!  CFX wrap token headers are 16 bytes.

KRB-PRIV and AP-REP are the PDUs with the shortest plaintext input to
encryption in RFC41210, I think.  If I count correctly a 0-byte
plaintext can yield a EncKrbPrivPart no shorter than exactly 23 bytes
assuming HostAddress types that are no shorter than 4 bytes.  As for
EncAPRepPart the ctime field (and its tags) along get us past 16
bytes.  Hmmm, an EncKrbCredPart with zero KrbCredInfoscould be shorter
than 16 bytes, but it'd be senseless.

That only leaves non-standard consumers of RFC3961 to worry about.

Nico
--

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From: Sam Hartman <hartmans-ietf@mit.edu>
To: Nico Williams <nico@cryptonector.com>
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In-Reply-To: <CAK3OfOhbf2CYgeCyJByXdwwcZfXegsK77nb=e1nQBATTJYsBcw@mail.gmail.com> (Nico Williams's message of "Fri, 24 May 2013 00:30:02 -0500")
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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>>>>> "Nico" == Nico Williams <nico@cryptonector.com> writes:

    Nico> On Thu, May 23, 2013 at 10:20 PM, Sam Hartman <hartmans-ietf@mit.edu> wrote:
    Nico> That only leaves non-standard consumers of RFC3961 to worry
    Nico> about.

    Nico> Nico --


    Jeff H has argued that those non-standard consumers are important.
I've seen no disagreement here.

As chair it sounds like we want to  fix the short-plaintext problem.

However, it's not sounding like it's going to come up in practice much.

I don't know that affects our decision space much, but it seems good to
characterize the problem we're solving.

we seem to need a solution to short plaintext because it is a
specification requirement.  It does not seem to be performance critical
or often-exercised code.

we also want to be careful not to have it be code that becomes often
exercised because its bugs are convenient for attackers:-)

From ghudson@mit.edu  Fri May 24 09:04:32 2013
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On 05/24/2013 08:44 AM, Sam Hartman wrote:
> As chair it sounds like we want to  fix the short-plaintext problem.
> 
> However, it's not sounding like it's going to come up in practice much.

Perhaps not with protocol data, but it comes up in MIT krb5 when
encrypting key data with the master key.  Encrypting a DES key in an AES
master key is a payload less than the block size (8 < 16); encrypting an
AES-128 key is a payload equal to the block size (16 = 16).

> we seem to need a solution to short plaintext because it is a
> specification requirement.  It does not seem to be performance critical
> or often-exercised code.

Decrypting key data is performance-relevant to KDCs, although my
experience is that for short payloads, API overhead competes with block
encryption costs.  Obviously, using RFC 3961 encryption for key data is
an implementation choice.

Also note that RFC 3962 has a short plaintext exception for 0-length
plaintexts--section 5 paragraphs 3 and 6.


From jhutz@cmu.edu  Fri May 24 11:40:15 2013
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Cc: kitten@ietf.org, Sam Hartman <hartmans-ietf@MIT.EDU>, jhutz@cmu.edu
Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Fri, 2013-05-24 at 12:04 -0400, Greg Hudson wrote:
> On 05/24/2013 08:44 AM, Sam Hartman wrote:
> > As chair it sounds like we want to  fix the short-plaintext problem.
> > 
> > However, it's not sounding like it's going to come up in practice much.
> 
> Perhaps not with protocol data, but it comes up in MIT krb5 when
> encrypting key data with the master key.  Encrypting a DES key in an AES
> master key is a payload less than the block size (8 < 16); encrypting an
> AES-128 key is a payload equal to the block size (16 = 16).
> 
> > we seem to need a solution to short plaintext because it is a
> > specification requirement.  It does not seem to be performance critical
> > or often-exercised code.
> 
> Decrypting key data is performance-relevant to KDCs, although my
> experience is that for short payloads, API overhead competes with block
> encryption costs.  Obviously, using RFC 3961 encryption for key data is
> an implementation choice.
> 
> Also note that RFC 3962 has a short plaintext exception for 0-length
> plaintexts--section 5 paragraphs 3 and 6.

RFC3962's discussion of CTS does indeed include a short plaintext
exception.  However, this never comes into play, because the enctypes
described in that document are based on the simplified profile, which
never invokes the underlying cipher with a message shorter than an
entire cipher block.  When encrypting application data, there is a
one-cipher-block confounder.  In key derivation, the constant is first
n-folded to the block size.  This turns out to be important, because key
derivation depends on the cipher behaving deterministically, and CTS as
described in RFC3962 section 5 is not required to behave
deterministically for inputs shorter than one block.


-- Jeff


From nico@cryptonector.com  Fri May 24 11:46:01 2013
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From: Nico Williams <nico@cryptonector.com>
To: Kelley Burgin <kwburgi@tycho.ncsc.mil>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Wed, May 22, 2013 at 10:51 AM, Nico Williams <nico@cryptonector.com> wrote:
> As for short-plaintext, I think I prefer Tom's counter mode solution
> (again, for performance reasons).

And also because it doesn't introduce any ambiguities for us to
resolve: if the ciphertext is shorter than 16 bytes then do the
counter mode thing, else do CTS.

Greg's note makes me nervous about abandoning short plaintext support.

Nico
--

From tlyu@mit.edu  Fri May 24 11:59:19 2013
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To: Nico Williams <nico@cryptonector.com>
References: <mailman.51.1368644424.24718.kitten@ietf.org> <44302EA3-1CB6-4F9A-A6B4-25F5FCDBCC0A@tycho.ncsc.mil> <ldvr4h1s2gi.fsf@cathode-dark-space.mit.edu> <CAK3OfOipm=J7vjwaLHvENuB8kKBo0GqZu1-YccRshY8nL4Pd8g@mail.gmail.com> <ldva9nprxm3.fsf@cathode-dark-space.mit.edu> <CAK3OfOjCHAUP6JuwNAmapcbEYADgOd3MjVcJk6MH+d-Pqf6NFA@mail.gmail.com> <ldvli79q8zy.fsf@cathode-dark-space.mit.edu> <22606_1369111554_r4L4jrrH023245_CAK3OfOiRsqC1RxbU96OGzOUj0=UEcQbXNKPrhBAgYyybQDHD_Q@mail.gmail.com> <1369154928.2711.772.camel@minbar.fac.cs.cmu.edu> <5F29C375-8261-41B2-B188-1938C6201ABD@tycho.ncsc.mil> <CAK3OfOgHbOxBUZDQbFYfX9hnLBMbioi4LZ9ccFEMU2A6Xn7cxw@mail.gmail.com> <9358351E-D3B6-49E3-B6B0-DDE71D95361C@tycho.ncsc.mil> <CAK3OfOig1C0E-g9wNZdnetsPoXLh73BLzNjHqHR52HGVRxQ-kQ@mail.gmail.com> <CAK3OfOhTVoij1_jC6Ej1_Eta1Tm=gyfV523fUL8+_19Zx5r5jQ@mail.gmail.com>
From: Tom Yu <tlyu@MIT.EDU>
Date: Fri, 24 May 2013 14:58:56 -0400
In-Reply-To: <CAK3OfOhTVoij1_jC6Ej1_Eta1Tm=gyfV523fUL8+_19Zx5r5jQ@mail.gmail.com> (Nico Williams's message of "Fri, 24 May 2013 13:45:49 -0500")
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Cc: kitten@ietf.org, Sam Hartman <hartmans-ietf@mit.edu>, "Kevin M. Igoe" <kmigoe@nsa.gov>, Jeffrey Hutzelman <jhutz@cmu.edu>
Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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Nico Williams <nico@cryptonector.com> writes:

> On Wed, May 22, 2013 at 10:51 AM, Nico Williams <nico@cryptonector.com> wrote:
>> As for short-plaintext, I think I prefer Tom's counter mode solution
>> (again, for performance reasons).
>
> And also because it doesn't introduce any ambiguities for us to
> resolve: if the ciphertext is shorter than 16 bytes then do the
> counter mode thing, else do CTS.

My suggestion didn't involve counter mode, just a different
interpretation of CTS.

From nico@cryptonector.com  Fri May 24 12:31:22 2013
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Date: Fri, 24 May 2013 14:30:50 -0500
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From: Nico Williams <nico@cryptonector.com>
To: Tom Yu <tlyu@mit.edu>
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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On Fri, May 24, 2013 at 1:58 PM, Tom Yu <tlyu@mit.edu> wrote:
> Nico Williams <nico@cryptonector.com> writes:
>> On Wed, May 22, 2013 at 10:51 AM, Nico Williams <nico@cryptonector.com> wrote:
>>> As for short-plaintext, I think I prefer Tom's counter mode solution
>>> (again, for performance reasons).
>>
>> And also because it doesn't introduce any ambiguities for us to
>> resolve: if the ciphertext is shorter than 16 bytes then do the
>> counter mode thing, else do CTS.
>
> My suggestion didn't involve counter mode, just a different
> interpretation of CTS.

Ah, I'd lost track.  Also, my approach doesn't have the ambiguity I
thought it had.

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Subject: Re: [kitten] Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00
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On 05/24/2013 02:40 PM, Jeffrey Hutzelman wrote:
> RFC3962's discussion of CTS does indeed include a short plaintext
> exception.  However, this never comes into play, because the enctypes
> described in that document are based on the simplified profile, which
> never invokes the underlying cipher with a message shorter than an
> entire cipher block.

But they can invoke the underlying cipher with a message length exactly
equal to one cipher block, if the RFC 3961 input length is zero.  So the
RFC 3962 exceptions for encrypting exactly one block can come into play.

(NIST SP800-38A is confusing on whether its algorithms are defined for
an input length of exactly one block.  The introductory text claims that
it specifies "three variants of CBC mode that accept any plaintext
input whose bit length is greater than or equal to the block size," but
the algorithms don't seem to work for an input equal to the block size.
 In CBC-CS1-Encrypt, for instance, you get n=1, d=b at step 1, a single
cipherblock C[1] at step 3, and then step 4 references C[0] which isn't
defined.)


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From: Thomas Hardjono <hardjono@MIT.EDU>
To: "kitten@ietf.org" <kitten@ietf.org>
Thread-Topic: [security- services] 30-day Public Review for SAML V2.0 Enhanced Client or Proxy Profile V2.0
Thread-Index: Ac5bxiUE6VtvRGhySvaBUambrl8XTQ==
Date: Tue, 28 May 2013 17:09:42 +0000
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Subject: [kitten] FW: [security- services] 30-day Public Review for SAML V2.0 Enhanced Client or Proxy Profile V2.0
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Dear Kitten WG,

This might be of interest to the Kitten WG.

/thomas/

____________________________________________



-----Original Message-----
From: security-services@lists.oasis-open.org [mailto:security-services@list=
s.oasis-open.org] On Behalf Of Chet Ensign
Sent: Thursday, May 23, 2013 11:06 AM
To: tc-announce@lists.oasis-open.org; members@lists.oasis-open.org; securit=
y-services@lists.oasis-open.org
Subject: [security-services] 30-day Public Review for SAML V2.0 Enhanced Cl=
ient or Proxy Profile V2.0

The OASIS Security Services (SAML) TC  [1] members have recently approved a=
 Committee Specification Draft (CSD) and submitted this specification for 3=
0-day public review:

SAML V2.0 Enhanced Client or Proxy Profile Version 2.0 Committee Specificat=
ion Draft 01 / Public Review Draft 01
14 May 2013

Specification Overview:

The SAML V2.0 Enhanced Client or Proxy profile is a Single Sign-On profile =
for use with HTTP, and clients with the capability to directly contact a pr=
incipal's identity provider(s) without requiring discovery and redirection =
by the service provider, as in the case of a browser. This specification up=
dates the original profile by adding support for "Holder of Key" subject co=
nfirmation and channel bindings, along with other miscellaneous features in=
 support of more advanced use cases.

Public Review Period:

The public review starts 23 May 2013 at 00:00 GMT and ends 22 June 2013 at =
23:59 GMT.

This is an open invitation to comment. OASIS solicits feedback from potenti=
al users, developers and others, whether OASIS members or not, for the sake=
 of improving the interoperability and quality of its technical work.

URIs:

The prose specification document and related files are available here:

Editable Source (Authoritative):
http://docs.oasis-open.org/security/saml/Post2.0/saml-ecp/v2.0/csprd01/saml=
-ecp-v2.0-csprd01.odt

HTML:
http://docs.oasis-open.org/security/saml/Post2.0/saml-ecp/v2.0/csprd01/saml=
-ecp-v2.0-csprd01.html

PDF:
http://docs.oasis-open.org/security/saml/Post2.0/saml-ecp/v2.0/csprd01/saml=
-ecp-v2.0-csprd01.pdf

XML schema:
http://docs.oasis-open.org/security/saml/Post2.0/saml-ecp/v2.0/csprd01/xsd/

ZIP distribution file (complete):

For your convenience, OASIS provides a complete package of the prose specif=
ication and related files in a ZIP distribution file. You can download the =
ZIP file here:

http://docs.oasis-open.org/security/saml/Post2.0/saml-ecp/v2.0/csprd01/saml=
-ecp-v2.0-csprd01.zip

Additional information about the specification and the OASIS Security Servi=
ces (SAML) TC can be found at the TC's public home page:

https://www.oasis-open.org/committees/security/

Comments may be submitted to the TC by any person through the use of the OA=
SIS TC Comment Facility which can be used by following the instructions on =
the TC's "Send A Comment" page, or directly at:

https://www.oasis-open.org/committees/comments/index.php?wg_abbrev=3Dsecuri=
ty

Comments submitted by TC non-members for this work and for other work of th=
is TC are publicly archived and can be viewed at:

https://lists.oasis-open.org/archives/security-services-comment/

All comments submitted to OASIS are subject to the OASIS Feedback License, =
which ensures that the feedback you provide carries the same obligations at=
 least as the obligations of the TC members. In connection with this public=
 review of "SAML V2.0 Enhanced Client or Proxy Profile V2.0", we call your =
attention to the OASIS IPR Policy [2] applicable especially [3] to the work=
 of this technical committee. All members of the TC should be familiar with=
 this document, which may create obligations regarding the disclosure and a=
vailability of a member's patent, copyright, trademark and license rights t=
hat read on an approved OASIS specification.

OASIS invites any persons who know of any such claims to disclose these if =
they may be essential to the implementation of the above specification, so =
that notice of them may be posted to the notice page for this TC's work.

=3D=3D=3D=3D=3D=3D=3D=3D=3D=3D Additional references:

[1] OASIS Security Services (SAML) TC
https://www.oasis-open.org/committees/security/

[2] http://www.oasis-open.org/who/intellectualproperty.php

[3] http://www.oasis-open.org/committees/security/ipr.php
https://www.oasis-open.org/policies-guidelines/ipr#s10.2.2
RF on RAND Mode

/chet
----------------
Chet Ensign
Director of Standards Development and TC Administration
OASIS: Advancing open standards for the information society http://www.oasi=
s-open.org

Primary: +1 973-996-2298
Mobile: +1 201-341-1393

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From hardjono@mit.edu  Tue May 28 10:11:14 2013
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From: Thomas Hardjono <hardjono@MIT.EDU>
To: "kitten@ietf.org" <kitten@ietf.org>
Thread-Topic: [security- services] 30-day Public Review for SAML V2.0 Channel Binding Extensions V1.0
Thread-Index: Ac5bxkREPl6EDJs/T3qX7pdqSTU3Zw==
Date: Tue, 28 May 2013 17:10:35 +0000
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Subject: [kitten] FW: [security- services] 30-day Public Review for SAML V2.0 Channel Binding Extensions V1.0
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Dear Kitten WG,

This might be of interest to the Kitten WG.

/thomas/

____________________________________________



-----Original Message-----
From: security-services@lists.oasis-open.org [mailto:security-services@list=
s.oasis-open.org] On Behalf Of Chet Ensign
Sent: Thursday, May 23, 2013 11:06 AM
To: tc-announce@lists.oasis-open.org; members@lists.oasis-open.org; securit=
y-services@lists.oasis-open.org
Subject: [security-services] 30-day Public Review for SAML V2.0 Channel Bin=
ding Extensions V1.0

The OASIS Security Services (SAML) TC  [1] members have recently approved a=
 Committee Specification Draft (CSD) and submitted this specification for 3=
0-day public review:

SAML V2.0 Channel Binding Extensions Version 1.0 Committee Specification Dr=
aft 01 / Public Review Draft 01
14 May 2013

Specification Overview:

This specification defines an extension to the SAML V2.0 protocol specifica=
tion that supports the use of channel bindings in conjunction with SAML pro=
files. It also includes a new SAML profile that applies the extension to a =
set of profiles that fit a particular communication pattern.

Public Review Period:

The public review starts 24 May 2013 at 00:00 GMT and ends 23 June 2013 at =
23:59 GMT.

This is an open invitation to comment. OASIS solicits feedback from potenti=
al users, developers and others, whether OASIS members or not, for the sake=
 of improving the interoperability and quality of its technical work.

URIs:

The prose specification document and related files are available here:

Editable Source (Authoritative):
http://docs.oasis-open.org/security/saml/Post2.0/saml-channel-binding-ext/v=
1.0/csprd01/saml-channel-binding-ext-v1.0-csprd01.odt

HTML:
http://docs.oasis-open.org/security/saml/Post2.0/saml-channel-binding-ext/v=
1.0/csprd01/saml-channel-binding-ext-v1.0-csprd01.html

PDF:
http://docs.oasis-open.org/security/saml/Post2.0/saml-channel-binding-ext/v=
1.0/csprd01/saml-channel-binding-ext-v1.0-csprd01.pdf

XML schema:
http://docs.oasis-open.org/security/saml/Post2.0/saml-channel-binding-ext/v=
1.0/csprd01/xsd/

ZIP distribution file (complete):

For your convenience, OASIS provides a complete package of the prose specif=
ication and related files in a ZIP distribution file. You can download the =
ZIP file here:

http://docs.oasis-open.org/security/saml/Post2.0/saml-channel-binding-ext/v=
1.0/csprd01/saml-channel-binding-ext-v1.0-csprd01.zip

Additional information about the specification and the OASIS Security Servi=
ces (SAML) TC can be found at the TC's public home page:

https://www.oasis-open.org/committees/security/

Comments may be submitted to the TC by any person through the use of the OA=
SIS TC Comment Facility which can be used by following the instructions on =
the TC's "Send A Comment" page, or directly at:

https://www.oasis-open.org/committees/comments/index.php?wg_abbrev=3Dsecuri=
ty

Comments submitted by TC non-members for this work and for other work of th=
is TC are publicly archived and can be viewed at:

https://lists.oasis-open.org/archives/security-services-comment/

All comments submitted to OASIS are subject to the OASIS Feedback License, =
which ensures that the feedback you provide carries the same obligations at=
 least as the obligations of the TC members. In connection with this public=
 review of "SAML V2.0 Channel Binding Extensions Version 1.0", we call your=
 attention to the OASIS IPR Policy [2] applicable especially [3] to the wor=
k of this technical committee. All members of the TC should be familiar wit=
h this document, which may create obligations regarding the disclosure and =
availability of a member's patent, copyright, trademark and license rights =
that read on an approved OASIS specification.

OASIS invites any persons who know of any such claims to disclose these if =
they may be essential to the implementation of the above specification, so =
that notice of them may be posted to the notice page for this TC's work.

=3D=3D=3D=3D=3D=3D=3D=3D=3D=3D Additional references:

[1] OASIS Security Services (SAML) TC
https://www.oasis-open.org/committees/security/

[2] http://www.oasis-open.org/who/intellectualproperty.php

[3] http://www.oasis-open.org/committees/security/ipr.php
https://www.oasis-open.org/policies-guidelines/ipr#s10.2.2
RF on RAND Mode

/chet
----------------
Chet Ensign
Director of Standards Development and TC Administration
OASIS: Advancing open standards for the information society http://www.oasi=
s-open.org

Primary: +1 973-996-2298
Mobile: +1 201-341-1393

---------------------------------------------------------------------
To unsubscribe from this mail list, you must leave the OASIS TC that genera=
tes this mail.  Follow this link to all your TCs in OASIS at:
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Subject: [kitten] Random-IV and short-plaintexts (Re: Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00)
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On Mon, May 20, 2013 at 5:37 PM, Tom Yu <tlyu@mit.edu> wrote:
> I think CTS will work if you are willing to modify the "IV" sent when
> the plaintext length is less than or equal to the block size;
> basically treat the IV as the next to last block of CBC ciphertext,
> truncating it to the length of the plaintext, and send the final block
> of CBC ciphertext as the "IV".

I really like this.  It might even be possible to minimize the code
path difference for short plaintexts too.

So the short-pt encryption case becomes:

 - pad pt with zeros
 - XOR with IV (cipherState XOR nonce)
 - encrypt (it's just ECB here, as it's only one block)
 - truncate the pad count of bytes from the ciphertext block and
replace the corresponding bytes of the nonce with those
 - apply the HMAC to the modified nonce and short ciphertext

The short-pt decryption case is trivial to work out from the above:

 - first verify the integrity tag
 - then reconstitute the block of ciphertext
 - decrypt
 - XOR with the nonce (which still has pad-count bytes from the ciphertext)
 - reconstitute the nonce (using pad-count bytes from the plaintext
resulting from the decryption)
 - update cipherState
 - truncate the plaintext to the original length

Note that 0-length and 1-block-long plaintexts are degenerate cases of
this.  And there's enough similarity to CTS that it might be possible
to make the code path differences for short and long plaintexts
minute.

Re-writing this to fit in section 6 notation:

   L(x) = length of x
   < = less-than operator; true == 1, false == 0
   zeroblock = one block (length c) of zeros
   o[start:len] = sub-string operation returning the substring of length
                  len of string o starting at byte start (zero-based)

encryption function       PC = (L(P) < c) * (c - L(P))
                          P' = P | zeroblock[0:PC]
                          N = random nonce of length c (128 bits)
                          IV = N XOR cipherState
                          C = E(Ke, P', IV)
                              using CBC-CS3-Encrypt defined
                              in [SP800-38A+]
                          N' = N[0:c - PC] | C[c - PC:PC]
                          H = HMAC(Ki, N' | C)
                          ciphertext =  N' | C | H[1..h]
                          cipherState = N

decryption function       (N', C, H) = ciphertext
                          PC = (L(C) < c) * (c - L(C))
                          if (H != HMAC(Ki, N' | C)[1..h])
                              stop, report error
                          if (PC > 0)
                              IV = zeroblock
                          else
                              IV = N' XOR cipherState
                          P' = D(Ke, C, IV)
                              using CBC-CS3-Decrypt defined
                              in [SP800-38A+]
                          if (PC > 0)
                              IV = (N'[0:c - PC] | P'[c - PC:PC])
                              N = IV XOR cipherState
                              P = (P' XOR IV)[0:c - PC]
                          else
                              P = P'
                              N = N'
                          cipherState = N

Style nit: the I-D refers to "cipher state", "cipherstate", and
"cipherState", but all seem to be the same thing.  This is confusing.
Pick a single spelling and stick with it.  I recommend "cipherState"
as that makes it clearer that we're talking about a quantity that's
specific to this enctype.

Style nit: using "+" to mean XOR and then having a parenthetical to
clarify this seems silly.  Might as well just say XOR :)

Nico
--

From kwburgi@tycho.ncsc.mil  Wed May 29 07:46:14 2013
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Subject: Re: [kitten] Random-IV and short-plaintexts (Re: Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00)
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This looks good to me, with a couple of comments below.=20

On May 28, 2013, at 3:34 PM, Nico Williams wrote:

> Re-writing this to fit in section 6 notation:
>=20
>   L(x) =3D length of x
>   < =3D less-than operator; true =3D=3D 1, false =3D=3D 0
>   zeroblock =3D one block (length c) of zeros
>   o[start:len] =3D sub-string operation returning the substring of =
length
>                  len of string o starting at byte start (zero-based)
>=20
> encryption function       PC =3D (L(P) < c) * (c - L(P))
>                          P' =3D P | zeroblock[0:PC]
>                          N =3D random nonce of length c (128 bits)
>                          IV =3D N XOR cipherState
>                          C =3D E(Ke, P', IV)
>                              using CBC-CS3-Encrypt defined
>                              in [SP800-38A+]
>                          N' =3D N[0:c - PC] | C[c - PC:PC]

Shouldn't you mac and send C[0:c - PC] instead of C? (L(C) =3D c since =
L(P') =3D c)

>                          H =3D HMAC(Ki, N' | C)
>                          ciphertext =3D  N' | C | H[1..h]
>                          cipherState =3D N
>=20
> decryption function       (N', C, H) =3D ciphertext
>                          PC =3D (L(C) < c) * (c - L(C))
>                          if (H !=3D HMAC(Ki, N' | C)[1..h])
>                              stop, report error
>                          if (PC > 0)
>                              IV =3D zeroblock
>                          else
>                              IV =3D N' XOR cipherState
>                          P' =3D D(Ke, C, IV)

If you do only send C[0:c - PC], you'll have to reconstruct C before you =
get here.
C' =3D C | N'[c - PC:PC]

>                              using CBC-CS3-Decrypt defined
>                              in [SP800-38A+]
>                          if (PC > 0)

Unless I've missed something, or confused myself with notation, at this =
point:
P' =3D P xor IV[0:c - PC] | IV[c - PC:PC]. (this is the real IV)

>                              IV =3D (N'[0:c - PC] | P'[c - PC:PC])

So here, IV =3D N[0:c - PC | IV[c - PC:PC]

>                              N =3D IV XOR cipherState

and here N =3D IV[0:c - PC] | N[c - PC:PC].

You could fix this by doing:
P'' =3D P' XOR cipherState (=3D P+N[0:c - PC] | N[c - PC:PC]
P =3D P''[0:c - PC] xor N'[0:c - PC] (these two lines could be combined =
into one)
N =3D (P | zeroblock[0:PC]) xor P''

>                              P =3D (P' XOR IV)[0:c - PC]
>                          else
>                              P =3D P'
>                              N =3D N'
>                          cipherState =3D N
>=20
> Style nit: the I-D refers to "cipher state", "cipherstate", and
> "cipherState", but all seem to be the same thing.  This is confusing.
> Pick a single spelling and stick with it.  I recommend "cipherState"
> as that makes it clearer that we're talking about a quantity that's
> specific to this enctype.
>=20
> Style nit: using "+" to mean XOR and then having a parenthetical to
> clarify this seems silly.  Might as well just say XOR :)

Sounds good - thanks.
>=20
> Nico
> --


From david.black@emc.com  Wed May 29 07:43:51 2013
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From: "Black, David" <david.black@emc.com>
To: "kitten@ietf.org" <kitten@ietf.org>
Date: Wed, 29 May 2013 10:43:04 -0400
Thread-Topic: Kerberos Considerations for iSCSI Authentication
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Subject: [kitten] Kerberos Considerations for iSCSI Authentication
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The storm WG's consolidated iSCSI draft (draft-ietf-storm-iscsi-cons-08)
has a few issues from IESG evaluation that need attention, one of which
is that some security considerations text for Kerberos needs to be added.
I don't know of any Kerberos authentication for iSCSI that's currently in
use, although it has been implemented at least once, and hence the
decision has been made to retain its specification as part of the iSCSI
protocol update in this draft.

I'd appreciate comments on the following text, and please at least cc:
me (preferably also the storm mailing list).  Note that KRB_AP_REQ
and KRB_AP_REP are the client message and server's response message
as defined in RFC 4120.

I do want to head off one area of comments - please send any "you
should use GSS-API" comments to /dev/null.  iSCSI was specified to use
Kerberos w/o GSS-API a long time ago, so GSS-API for iSCSI would be a
new iSCSI authentication mechanism that should be in a separate draft,
as opposed to this update (which is already long enough).

------------------

9.2.3 Kerberos Considerations for iSCSI Authentication
=20
iSCSI uses Kerberos via "bare" tokens - i.e. does not use GSS-API ([RFC4121=
]) -
for authenticating the two Kerberos principals during the iSCSI Login proce=
ss.
This implies that iSCSI implementations supporting the KRB5 AuthMethod
(Section 12.1) are directly involved in the Kerberos protocol. Specifically=
,
the following actions MUST be performed as specified in [RFC4120]:

          - Target MUST validate the KRB_AP_REQ to ensure that the
			initiator can be trusted
          - When mutual authentication is selected, the initiator
			MUST validate KRB_AP_REP

to determine the outcome of mutual authentication
=20
As Kerberos V5 is capable of providing mutual authentication, implementatio=
ns
SHOULD support mutual authentication by default for login authentication.
Note however that Kerberos authentication only assures that the server
(iSCSI target) can be trusted by the Kerberos client (initiator) and
vice-versa; an initiator should employ appropriately secured service
discovery techniques (e.g. iSNS, Section 4.2.7) to ensure that it is
talking to the intended target principal.

------------------

Thanks,
--David (storm WG co-chair)
----------------------------------------------------
David L. Black, Distinguished Engineer
EMC Corporation, 176 South St., Hopkinton, MA=A0 01748
+1 (508) 293-7953=A0=A0=A0=A0=A0=A0=A0=A0=A0=A0=A0=A0 FAX: +1 (508) 293-778=
6
david.black@emc.com=A0=A0=A0=A0=A0=A0=A0 Mobile: +1 (978) 394-7754
----------------------------------------------------



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On Wed, May 29, 2013 at 9:50 AM, Kelley Burgin <kwburgi@tycho.ncsc.mil> wrote:
> This looks good to me, with a couple of comments below.

Oh dear, I meant to define C' and use that in the HMAC input.  Dunno
how I forgot.

> On May 28, 2013, at 3:34 PM, Nico Williams wrote:
>
>> Re-writing this to fit in section 6 notation:
>>
>>   L(x) = length of x
>>   < = less-than operator; true == 1, false == 0
>>   zeroblock = one block (length c) of zeros
>>   o[start:len] = sub-string operation returning the substring of length
>>                  len of string o starting at byte start (zero-based)
>>
>> encryption function       PC = (L(P) < c) * (c - L(P))
>>                          P' = P | zeroblock[0:PC]
>>                          N = random nonce of length c (128 bits)
>>                          IV = N XOR cipherState
>>                          C = E(Ke, P', IV)
>>                              using CBC-CS3-Encrypt defined
>>                              in [SP800-38A+]
>>                          N' = N[0:c - PC] | C[c - PC:PC]
>
> Shouldn't you mac and send C[0:c - PC] instead of C? (L(C) = c since L(P') = c)

Yes.  I got sloppy there.

+>>                          C' = C[0:c - PC]
->>                          H = HMAC(Ki, N' | C)
+>>                          H = HMAC(Ki, N' | C')

->>                          ciphertext =  N' | C | H[1..h]
+>>                          ciphertext =  N' | C' | H[1..h]
>>                          cipherState = N

I also had to be consistent about matching ' usage in the encrypt and
decrypt side.  Let's make N', P', and C' match on both side, and let's
add an IV' on the decrypt side

->>decryption function       (N', C, H) = ciphertext
+>>decryption function       (N', C', H) = ciphertext
->>                          PC = (L(C) < c) * (c - L(C))
+>>                          PC = (L(C') < c) * (c - L(C'))
->>                          if (H != HMAC(Ki, N' | C)[1..h])
+>>                          if (H != HMAC(Ki, N' | C')[1..h])
 >>                              stop, report error
 >>                          if (PC > 0)
->>                              IV = zeroblock
+>>                              IV' = zeroblock
+>>                              C = C' | N[c - PC:PC]
 >>                          else
 >>                              IV = N' XOR cipherState
+>>                              C = C'
 >>                          P' = D(Ke, C, IV)
+>>                          if (PC > 0)
 >>                              P = P'[0:c - PC]
 >>                          else

> Unless I've missed something, or confused myself with notation, at this point:
> P' = P xor IV[0:c - PC] | IV[c - PC:PC]. (this is the real IV)
>
>>                              IV = (N'[0:c - PC] | P'[c - PC:PC])
>
> So here, IV = N[0:c - PC | IV[c - PC:PC]

Earlier if PC > 0 we set IV to be the zeroblock, so that's not quite
right.  We're reversing the encryption side where we encrypted a
zero-padded plaintext, and since XOR zero is the identity function the
trailing c-PC:PC bytes of P' will be the trailing bytes of the
original IV (which we still need so we can recover N and update the
cipherState).

Let me see if I can put this together without errors this time, and
maybe I can clarify the IV recovery:

   L(x) = length of x
   < = less-than operator; true == 1, false == 0
   zeroblock = one block (length c) of zeros
   o[start:len] = sub-string operation returning the substring of length
                  len of string o starting at byte start (zero-based)

encryption function       PC = (L(P) < c) * (c - L(P))
                          P' = P | zeroblock[0:PC]
                          N = random nonce of length c (128 bits)
                          IV = N XOR cipherState
                          C = E(Ke, P', IV)
                              using CBC-CS3-Encrypt defined
                              in [SP800-38A+]
                          N' = N[0:c - PC] | C[c - PC:PC]
                          C' = C[0:c - PC]
                          H = HMAC(Ki, N' | C')
                          ciphertext =  N' | C' | H[1..h]
                          cipherState = N

decryption function       (N', C', H) = ciphertext
                          PC = (L(C') < c) * (c - L(C'))
                          if (H != HMAC(Ki, N' | C')[1..h])
                              stop, report error
                          if (PC > 0)
                              IV' = zeroblock
                              C = C' | N[c - PC:PC]
                          else
                              IV' = N' XOR cipherState
                              C = C'
                          P' = D(Ke, C, IV')
                              using CBC-CS3-Decrypt defined
                              in [SP800-38A+]
                          if (PC > 0)
                              // IV = (N'[0:c - PC] | zeroblock[c - PC:PC]) XOR
                              //      (zeroblock[0:c - PC] | P'[c - PC:PC])
                              IV = (N'[0:c - PC] | P'[c - PC:PC])
                              N = IV XOR cipherState
                              P = (P' XOR IV)[0:c - PC]
                          else
                              IV = IV'   // but we no longer need this
                              P = P'
                              N = N'
                          cipherState = N

The decrypt side is tricky to get right :)

Have at it.  I'm sure I still slipped up.

Nico
--

From kwburgi@tycho.ncsc.mil  Wed May 29 10:32:01 2013
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Subject: Re: [kitten] Random-IV and short-plaintexts (Re: Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00)
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I still have a question about the decrypt: seems like=20

IV =3D (N'[0:c - PC] | P'[c - PC:PC]) is really N[0:c - PC] | IV[c - =
PC:PC]), not the original IV. Did I miss something?=20

As you point out, we don't actually need to recover the IV (just N), so =
we can compute the plaintext P directly from P' by (if I didn't mess =
up):

P =3D (P' XOR cipherState XOR N')[0:c - PC]


On May 29, 2013, at 1:14 PM, Nico Williams wrote:

> On Wed, May 29, 2013 at 9:50 AM, Kelley Burgin =
<kwburgi@tycho.ncsc.mil> wrote:
>> This looks good to me, with a couple of comments below.
>=20
> Oh dear, I meant to define C' and use that in the HMAC input.  Dunno
> how I forgot.
>=20
>> On May 28, 2013, at 3:34 PM, Nico Williams wrote:
>>=20
>>> Re-writing this to fit in section 6 notation:
>>>=20
>>>  L(x) =3D length of x
>>>  < =3D less-than operator; true =3D=3D 1, false =3D=3D 0
>>>  zeroblock =3D one block (length c) of zeros
>>>  o[start:len] =3D sub-string operation returning the substring of =
length
>>>                 len of string o starting at byte start (zero-based)
>>>=20
>>> encryption function       PC =3D (L(P) < c) * (c - L(P))
>>>                         P' =3D P | zeroblock[0:PC]
>>>                         N =3D random nonce of length c (128 bits)
>>>                         IV =3D N XOR cipherState
>>>                         C =3D E(Ke, P', IV)
>>>                             using CBC-CS3-Encrypt defined
>>>                             in [SP800-38A+]
>>>                         N' =3D N[0:c - PC] | C[c - PC:PC]
>>=20
>> Shouldn't you mac and send C[0:c - PC] instead of C? (L(C) =3D c =
since L(P') =3D c)
>=20
> Yes.  I got sloppy there.
>=20
> +>>                          C' =3D C[0:c - PC]
> ->>                          H =3D HMAC(Ki, N' | C)
> +>>                          H =3D HMAC(Ki, N' | C')
>=20
> ->>                          ciphertext =3D  N' | C | H[1..h]
> +>>                          ciphertext =3D  N' | C' | H[1..h]
>>>                         cipherState =3D N
>=20
> I also had to be consistent about matching ' usage in the encrypt and
> decrypt side.  Let's make N', P', and C' match on both side, and let's
> add an IV' on the decrypt side
>=20
> ->>decryption function       (N', C, H) =3D ciphertext
> +>>decryption function       (N', C', H) =3D ciphertext
> ->>                          PC =3D (L(C) < c) * (c - L(C))
> +>>                          PC =3D (L(C') < c) * (c - L(C'))
> ->>                          if (H !=3D HMAC(Ki, N' | C)[1..h])
> +>>                          if (H !=3D HMAC(Ki, N' | C')[1..h])
>>>                             stop, report error
>>>                         if (PC > 0)
> ->>                              IV =3D zeroblock
> +>>                              IV' =3D zeroblock
> +>>                              C =3D C' | N[c - PC:PC]
>>>                         else
>>>                             IV =3D N' XOR cipherState
> +>>                              C =3D C'
>>>                         P' =3D D(Ke, C, IV)
> +>>                          if (PC > 0)
>>>                             P =3D P'[0:c - PC]
>>>                         else
>=20
>> Unless I've missed something, or confused myself with notation, at =
this point:
>> P' =3D P xor IV[0:c - PC] | IV[c - PC:PC]. (this is the real IV)
>>=20
>>>                             IV =3D (N'[0:c - PC] | P'[c - PC:PC])
>>=20
>> So here, IV =3D N[0:c - PC | IV[c - PC:PC]
>=20
> Earlier if PC > 0 we set IV to be the zeroblock, so that's not quite
> right.  We're reversing the encryption side where we encrypted a
> zero-padded plaintext, and since XOR zero is the identity function the
> trailing c-PC:PC bytes of P' will be the trailing bytes of the
> original IV (which we still need so we can recover N and update the
> cipherState).
>=20
> Let me see if I can put this together without errors this time, and
> maybe I can clarify the IV recovery:
>=20
>   L(x) =3D length of x
>   < =3D less-than operator; true =3D=3D 1, false =3D=3D 0
>   zeroblock =3D one block (length c) of zeros
>   o[start:len] =3D sub-string operation returning the substring of =
length
>                  len of string o starting at byte start (zero-based)
>=20
> encryption function       PC =3D (L(P) < c) * (c - L(P))
>                          P' =3D P | zeroblock[0:PC]
>                          N =3D random nonce of length c (128 bits)
>                          IV =3D N XOR cipherState
>                          C =3D E(Ke, P', IV)
>                              using CBC-CS3-Encrypt defined
>                              in [SP800-38A+]
>                          N' =3D N[0:c - PC] | C[c - PC:PC]
>                          C' =3D C[0:c - PC]
>                          H =3D HMAC(Ki, N' | C')
>                          ciphertext =3D  N' | C' | H[1..h]
>                          cipherState =3D N
>=20
> decryption function       (N', C', H) =3D ciphertext
>                          PC =3D (L(C') < c) * (c - L(C'))
>                          if (H !=3D HMAC(Ki, N' | C')[1..h])
>                              stop, report error
>                          if (PC > 0)
>                              IV' =3D zeroblock
>                              C =3D C' | N[c - PC:PC]
>                          else
>                              IV' =3D N' XOR cipherState
>                              C =3D C'
>                          P' =3D D(Ke, C, IV')
>                              using CBC-CS3-Decrypt defined
>                              in [SP800-38A+]
>                          if (PC > 0)
>                              // IV =3D (N'[0:c - PC] | zeroblock[c - =
PC:PC]) XOR
>                              //      (zeroblock[0:c - PC] | P'[c - =
PC:PC])
>                              IV =3D (N'[0:c - PC] | P'[c - PC:PC])
>                              N =3D IV XOR cipherState
>                              P =3D (P' XOR IV)[0:c - PC]
>                          else
>                              IV =3D IV'   // but we no longer need =
this
>                              P =3D P'
>                              N =3D N'
>                          cipherState =3D N
>=20
> The decrypt side is tricky to get right :)
>=20
> Have at it.  I'm sure I still slipped up.
>=20
> Nico
> --


From nico@cryptonector.com  Wed May 29 10:50:03 2013
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Subject: Re: [kitten] Random-IV and short-plaintexts (Re: Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00)
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On Wed, May 29, 2013 at 12:35 PM, Kelley Burgin <kwburgi@tycho.ncsc.mil> wrote:
> I still have a question about the decrypt: seems like
>
> IV = (N'[0:c - PC] | P'[c - PC:PC]) is really N[0:c - PC] | IV[c - PC:PC]), not the original IV. Did I miss something?

IV is not set at this point, so we can't refer to it in computing it.
And IV' is the zeroblock in the case of short-plaintexts.

> As you point out, we don't actually need to recover the IV (just N), so we can compute the plaintext P directly from P' by (if I didn't mess up):
>
> P = (P' XOR cipherState XOR N')[0:c - PC]

We don't need to recover IV as a discrete element in this case.  We do
need to update cipherState, and there's simple re-writes of the above
pseudo-code; I thought my verbose rendition should be preferable to
something more concise, but maybe concise is better?

From kwburgi@tycho.ncsc.mil  Wed May 29 11:04:58 2013
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Subject: Re: [kitten] Random-IV and short-plaintexts (Re: Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00)
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All this notation is confusing...

I was meaning to say that when you decrypt C using the all zeros IV', =
the value you get out is=20

P' =3D (P XOR N[0:c - PC] XOR cipherState[0:c - PC]) | (N[c - PC:PC] XOR =
cipherState[c - PC:PC])

and=20

N' =3D N[0:c - PC] | C[c - PC:PC]

where N is the nonce generated by the encryptor.

So to define IV =3D N'[0:c - PC] | P'[c - PC:PC] will not define the =
same IV the encryptor used.

On May 29, 2013, at 1:49 PM, Nico Williams wrote:

> On Wed, May 29, 2013 at 12:35 PM, Kelley Burgin =
<kwburgi@tycho.ncsc.mil> wrote:
>> I still have a question about the decrypt: seems like
>>=20
>> IV =3D (N'[0:c - PC] | P'[c - PC:PC]) is really N[0:c - PC] | IV[c - =
PC:PC]), not the original IV. Did I miss something?
>=20
> IV is not set at this point, so we can't refer to it in computing it.
> And IV' is the zeroblock in the case of short-plaintexts.
>=20
>> As you point out, we don't actually need to recover the IV (just N), =
so we can compute the plaintext P directly from P' by (if I didn't mess =
up):
>>=20
>> P =3D (P' XOR cipherState XOR N')[0:c - PC]
>=20
> We don't need to recover IV as a discrete element in this case.  We do
> need to update cipherState, and there's simple re-writes of the above
> pseudo-code; I thought my verbose rendition should be preferable to
> something more concise, but maybe concise is better?


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Subject: Re: [kitten] Random-IV and short-plaintexts (Re: Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00)
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--f46d043be27a09e74e04dddf7c60
Content-Type: text/plain; charset=UTF-8

On May 29, 2013 1:04 PM, "Kelley Burgin" <kwburgi@tycho.ncsc.mil> wrote:
>
> All this notation is confusing...
>
> I was meaning to say that when you decrypt C using the all zeros IV', the
value you get out is
>
> P' = (P XOR N[0:c - PC] XOR cipherState[0:c - PC]) | (N[c - PC:PC] XOR
cipherState[c - PC:PC])
>
> and
>
> N' = N[0:c - PC] | C[c - PC:PC]
>
> where N is the nonce generated by the encryptor.
>
> So to define IV = N'[0:c - PC] | P'[c - PC:PC] will not define the same
IV the encryptor used.

Right, but it's just XORed after the one block operation, so we can fix it
with another XOR.  I didn't want to use an E() with no IV, that's all :)

--f46d043be27a09e74e04dddf7c60
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<p dir=3D"ltr"><br>
On May 29, 2013 1:04 PM, &quot;Kelley Burgin&quot; &lt;<a href=3D"mailto:kw=
burgi@tycho.ncsc.mil">kwburgi@tycho.ncsc.mil</a>&gt; wrote:<br>
&gt;<br>
&gt; All this notation is confusing...<br>
&gt;<br>
&gt; I was meaning to say that when you decrypt C using the all zeros IV&#3=
9;, the value you get out is<br>
&gt;<br>
&gt; P&#39; =3D (P XOR N[0:c - PC] XOR cipherState[0:c - PC]) | (N[c - PC:P=
C] XOR cipherState[c - PC:PC])<br>
&gt;<br>
&gt; and<br>
&gt;<br>
&gt; N&#39; =3D N[0:c - PC] | C[c - PC:PC]<br>
&gt;<br>
&gt; where N is the nonce generated by the encryptor.<br>
&gt;<br>
&gt; So to define IV =3D N&#39;[0:c - PC] | P&#39;[c - PC:PC] will not defi=
ne the same IV the encryptor used.</p>
<p dir=3D"ltr">Right, but it&#39;s just XORed after the one block operation=
, so we can fix it with another XOR.=C2=A0 I didn&#39;t want to use an E() =
with no IV, that&#39;s all :)</p>

--f46d043be27a09e74e04dddf7c60--

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Subject: Re: [kitten] Random-IV and short-plaintexts (Re: Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00)
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On Wed, May 29, 2013 at 1:23 PM, Nico Williams <nico@cryptonector.com> wrote:
> Right, but it's just XORed after the one block operation, so we can fix it
> with another XOR.  I didn't want to use an E() with no IV, that's all :)

Let me try to write clearer pseudo-code, but also more verbose :(  And
yes, there had been two bugs that I just noticed: 1) the encrypt side
didn't quite handle non-short plaintexts, 2) I was missing an XOR of
cipherState in the decrypt side.


   L(x) = length of x
   < = less-than operator; true == 1, false == 0
   zeroblock = one block (length c) of zeros
   o[start:len] = sub-string operation returning the substring of length
                  len of string o starting at byte start (zero-based)

encryption function
                      if (L(P) >= c)
                          PC = 0
                          P' = P
                      else
                          PC = c - L(P)
                          P' = P | zeroblock[0:PC]
                      N = random nonce of length c (128 bits)
                      IV = N XOR cipherState
                      C = E(Ke, P', IV)
                          // using CBC-CS3-Encrypt defined
                          // in [SP800-38A+]
                      if (PC > 0)
                          N' = N[0:c - PC] | C[c - PC:PC]
                          C' = C[0:c - PC]
                      else
                          N' = N
                          C' = C
                      H = HMAC(Ki, N' | C')
                      ciphertext =  N' | C' | H[1..h]
                      cipherState = N


decryption function
                      (N', C', H) = ciphertext
                      if (H != HMAC(Ki, N' | C')[1..h])
                          stop, report error

                      if (L(C') >= c)
                          // Not short-plaintext
                          IV = N' XOR cipherState
                          P = D(Ke, C', IV)
                              // using CBC-CS3-Decrypt defined
                              // in [SP800-38A+]
                          cipherState = N'
                          stop, output P, success

                      // Short plaintext
                      PC = c - L(C')
                      C = C' | N[c - PC:PC]
                      P' = D(Ke, C, zeroblock) // basically no IV
                           // using CBC-CS3-Decrypt defined
                           // in [SP800-38A+], but equivalent to ECB
                           // with no IV; we have to fix up P' below
                      // We need to compute the IV to recover P
                      // with and cipherState
                      //
                      // N' had been N[0:c - PC] | C[c - PC:PC] and
                      // we'd taken c-PC bytes from the original N to
                      // make P'.  First we reconstruct N:
                      N = N'[0:c - PC] | P'[c - PC:PC]

                      // Then use N to recover the IV (as above)
                      IV = N XOR cipherState

                      // XOR P' with the IV (because we used a zero IV
                      // in D above, so we have to handle that here;
                      // it's just one block, so this works), truncate
                      // the result, and update the cipherState
                      P = (P' XOR IV)[0:c - PC]
                      cipherState = N
                      stop, output P, success

From nico@cryptonector.com  Wed May 29 13:18:00 2013
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Date: Wed, 29 May 2013 15:15:32 -0500
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From: Nico Williams <nico@cryptonector.com>
To: "Black, David" <david.black@emc.com>
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Subject: Re: [kitten] Kerberos Considerations for iSCSI Authentication
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On Wed, May 29, 2013 at 9:43 AM, Black, David <david.black@emc.com> wrote:
> I do want to head off one area of comments - please send any "you
> should use GSS-API" comments to /dev/null.  iSCSI was specified to use
> Kerberos w/o GSS-API a long time ago, so GSS-API for iSCSI would be a
> new iSCSI authentication mechanism that should be in a separate draft,
> as opposed to this update (which is already long enough).

Other comments to head of:

 - Kebreros <-> IPsec binding?  never mind; we failed to get uptake on RFC5660.

> ------------------
>
> 9.2.3 Kerberos Considerations for iSCSI Authentication
>
> iSCSI uses Kerberos via "bare" tokens - i.e. does not use GSS-API ([RFC4121]) -
> for authenticating the two Kerberos principals during the iSCSI Login process.

s/tokens/PDUs/  (and define the term: Protocol Data Unit).  Or better:

NEW:
   iSCSI uses raw Kerberos V5 [RFC4120] for authenticating a client
(iSCSI initiator) principal to a service (iSCSI target) principal.
Note that iSCSI does not use the Generic Security Services Application
Programming Interface (GSS-API) [RFC2743] nor the Kerberos V5 GSS-API
security mechanism [RFC4121].

> This implies that iSCSI implementations supporting the KRB5 AuthMethod
> (Section 12.1) are directly involved in the Kerberos protocol. Specifically,
> the following actions MUST be performed as specified in [RFC4120]:

The first sentence of the above para says nothing to me :(  Remove it?

>           - Target MUST validate the KRB_AP_REQ to ensure that the
>                         initiator can be trusted
>           - When mutual authentication is selected, the initiator
>                         MUST validate KRB_AP_REP
> to determine the outcome of mutual authentication

Yes.  (Assuming there's text elsewhere saying that these PDUs have to
be sent and received in order to validate them :)

> As Kerberos V5 is capable of providing mutual authentication, implementations
> SHOULD support mutual authentication by default for login authentication.

Is there a reason not to make this a MUST?

> Note however that Kerberos authentication only assures that the server
> (iSCSI target) can be trusted by the Kerberos client (initiator) and
> vice-versa; an initiator should employ appropriately secured service
> discovery techniques (e.g. iSNS, Section 4.2.7) to ensure that it is
> talking to the intended target principal.

Some text somewhere should note that Kerberos is not used to provide
integrity nor confidentiality protection to the iSCSI protocol (and
that only IPsec does, and so on).

Nico
--

From nico@cryptonector.com  Wed May 29 14:28:44 2013
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From: Nico Williams <nico@cryptonector.com>
To: Kelley Burgin <kwburgi@tycho.ncsc.mil>
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Subject: Re: [kitten] Random-IV and short-plaintexts (Re: Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00)
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Greg points out that for the short plaintext case I really have to
clarify that E() and D() are ECB mode.

   L(x) = length of x
   < = less-than operator; true == 1, false == 0
   zeroblock = one block (length c) of zeros
   o[start:len] = sub-string operation returning the substring of length
                  len of string o starting at byte start (zero-based)

encryption function
                      N = random nonce of length c (128 bits)
                      IV = N XOR cipherState
                      if (L(P) > c)
                          PC = 0
                          P' = P
                          C = E(Ke, P', IV)
                              // using CBC-CS3-Encrypt defined
                              // in [SP800-38A+]
                          N' = N
                          C' = C
                      else
                          PC = c - L(P)
                          P' = P | zeroblock[0:PC]
                          C = E(Ke, P' XOR IV)
                              // using ECB mode
                          N' = N[0:c - PC] | C[c - PC:PC]
                          C' = C[0:c - PC]
                      H = HMAC(Ki, N' | C')
                      ciphertext =  N' | C' | H[1..h]
                      cipherState = N


decryption function
                      (N', C', H) = ciphertext
                      if (H != HMAC(Ki, N' | C')[1..h])
                          stop, report error

                      if (L(C') >= c)
                          // Not short-plaintext
                          IV = N' XOR cipherState
                          P = D(Ke, C', IV)
                              // using CBC-CS3-Decrypt defined
                              // in [SP800-38A+]
                          cipherState = N'
                          stop, output P, success

                      // Short plaintext
                      PC = c - L(C')
                      C = C' | N[c - PC:PC]
                      P' = D(Ke, C)
                           // using ECB mode

                      // We need to compute the IV to recover P
                      // with and cipherState
                      //
                      // N' had been N[0:c - PC] | C[c - PC:PC] and
                      // we'd taken c-PC bytes from the original N to
                      // make P'.  First we reconstruct N:
                      N = N'[0:c - PC] | P'[c - PC:PC]

                      // Then use N to recover the IV (as above)
                      IV = N XOR cipherState

                      // XOR P' with the IV (because we used a zero IV
                      // in D above, so we have to handle that here;
                      // it's just one block, so this works), truncate
                      // the result, and update the cipherState
                      P = (P' XOR IV)[0:c - PC]
                      cipherState = N
                      stop, output P, success

From david.black@emc.com  Wed May 29 17:18:59 2013
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From: "Black, David" <david.black@emc.com>
To: Nico Williams <nico@cryptonector.com>
Date: Wed, 29 May 2013 20:18:33 -0400
Thread-Topic: [kitten] Kerberos Considerations for iSCSI Authentication
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From: Nico Williams <nico@cryptonector.com>
To: Kelley Burgin <kwburgi@tycho.ncsc.mil>
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Subject: Re: [kitten] Random-IV and short-plaintexts (Re: Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00)
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Kelly points out that the decrypt side I posted doesn't update
cipherState properly and offers example inputs to work the code
through.  This should fix it (example below):

decryption function
                      (N', C', H) = ciphertext
                      if (H != HMAC(Ki, N' | C')[1..h])
                          stop, report error

                      if (L(C') >= c)
                          // Not short-plaintext
                          IV = N' XOR cipherState
                          P = D(Ke, C', IV)
                              // using CBC-CS3-Decrypt defined
                              // in [SP800-38A+]
                          cipherState = N'
                          stop, output P, success

                      // Short plaintext
                      PC = c - L(C')
                      C = C' | N[c - PC:PC]
                      P' = D(Ke, C)
                           // using ECB mode

                      // P' here == (P | zeroblock[0:PC]) XOR IV
                      // so IV[c - PC:PC] == P'[c - PC:PC]
                      // In the non-short-pt case we'd recover
                      // IV as N XOR cipherState, but here we only know
                      // a head of N and tail of IV.

                      N = N'[0:c -PC] | (P' XOR cipherState)[c - PC:PC]
                      IV = N XOR cipherState


                      P = (P' XOR IV)[0:PC]
                      cipherState = N
                      stop, output P, success

Kelly proposes that we "suppose P = 1111, N = 10101010...., and
cipherState = 010101010.... so that IV = 1111111.... (where the ...
means the pattern repeats to fill out the block). Then the value
encrypted is P+IV = 000011111111... which is the same value the
decryptor ends up with as P'. N' is also defined to be 1010******
where the ***** is ciphertext".

In Kelly's example PC = 12 (16 - 4).  We need substring operations
[0:4] and [4:12]

So on the decrypt side N[0:4] == 1010, P'[0:4] = 0000, while P'[4:12]
== 111111... == IV[4:12].  We have to recover either N[4:12] or
IV[0:4], and then we can recover the other by XORing with cipherState.
 With the above pseudo code then we have:

   N = 1010 | (1111... XOR cipherState)[4:12]
   N = 1010 | 1111...[4:12] XOR 0101...[4:12]
   N = 10101010...
   IV = N XOR cipherState == 1111...
   P = (P' XOR IV)[0:4] == 11110000...[0:4] == 1111

So we recover the P correctly, and because we recover N correctly we
then set cipherState correctly.

Note that this:

   N = N'[0:PC] | (P' XOR cipherState)[c - PC:PC]
   IV = N XOR cipherState

is equivalent to this:

   IV = (N' XOR cipherState)[0:PC] | P'[c - PC:PC]
   N = IV XOR cipherState

If we plug data into that we get:

   IV = (1010****... XOR cipherState)[0:4] | P'[4:12]
   IV = 1010 XOR 0101 | 1111...
   IV = 1111 | 1111... == 1111..
   N = 1111... XOR 0101... == 1010...

and then P and cipherState come out the same as above.

Nico
--

From kwburgi@tycho.ncsc.mil  Fri May 31 08:56:02 2013
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To: Nico Williams <nico@cryptonector.com>
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Subject: Re: [kitten] Random-IV and short-plaintexts (Re: Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00)
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This looks great.=20

Last comment (I think): The encrypt side considers the case L(P) =3D c =
to be short-plaintext, whereas the decrypt side considers it not short =
("L(P) > c" vs "L(C') >=3D c").=20

Also, guess C =3D C' | N[c - PC:PC] in the short-plaintext decrypt =
should use N'.

Kelley

On May 30, 2013, at 3:57 PM, Nico Williams wrote:

> Kelly points out that the decrypt side I posted doesn't update
> cipherState properly and offers example inputs to work the code
> through.  This should fix it (example below):
>=20
> decryption function
>                      (N', C', H) =3D ciphertext
>                      if (H !=3D HMAC(Ki, N' | C')[1..h])
>                          stop, report error
>=20
>                      if (L(C') >=3D c)
>                          // Not short-plaintext
>                          IV =3D N' XOR cipherState
>                          P =3D D(Ke, C', IV)
>                              // using CBC-CS3-Decrypt defined
>                              // in [SP800-38A+]
>                          cipherState =3D N'
>                          stop, output P, success
>=20
>                      // Short plaintext
>                      PC =3D c - L(C')
>                      C =3D C' | N[c - PC:PC]
>                      P' =3D D(Ke, C)
>                           // using ECB mode
>=20
>                      // P' here =3D=3D (P | zeroblock[0:PC]) XOR IV
>                      // so IV[c - PC:PC] =3D=3D P'[c - PC:PC]
>                      // In the non-short-pt case we'd recover
>                      // IV as N XOR cipherState, but here we only know
>                      // a head of N and tail of IV.
>=20
>                      N =3D N'[0:c -PC] | (P' XOR cipherState)[c - =
PC:PC]
>                      IV =3D N XOR cipherState
>=20
>=20
>                      P =3D (P' XOR IV)[0:PC]
>                      cipherState =3D N
>                      stop, output P, success
>=20
> Kelly proposes that we "suppose P =3D 1111, N =3D 10101010...., and
> cipherState =3D 010101010.... so that IV =3D 1111111.... (where the =
...
> means the pattern repeats to fill out the block). Then the value
> encrypted is P+IV =3D 000011111111... which is the same value the
> decryptor ends up with as P'. N' is also defined to be 1010******
> where the ***** is ciphertext".
>=20
> In Kelly's example PC =3D 12 (16 - 4).  We need substring operations
> [0:4] and [4:12]
>=20
> So on the decrypt side N[0:4] =3D=3D 1010, P'[0:4] =3D 0000, while =
P'[4:12]
> =3D=3D 111111... =3D=3D IV[4:12].  We have to recover either N[4:12] =
or
> IV[0:4], and then we can recover the other by XORing with cipherState.
> With the above pseudo code then we have:
>=20
>   N =3D 1010 | (1111... XOR cipherState)[4:12]
>   N =3D 1010 | 1111...[4:12] XOR 0101...[4:12]
>   N =3D 10101010...
>   IV =3D N XOR cipherState =3D=3D 1111...
>   P =3D (P' XOR IV)[0:4] =3D=3D 11110000...[0:4] =3D=3D 1111
>=20
> So we recover the P correctly, and because we recover N correctly we
> then set cipherState correctly.
>=20
> Note that this:
>=20
>   N =3D N'[0:PC] | (P' XOR cipherState)[c - PC:PC]
>   IV =3D N XOR cipherState
>=20
> is equivalent to this:
>=20
>   IV =3D (N' XOR cipherState)[0:PC] | P'[c - PC:PC]
>   N =3D IV XOR cipherState
>=20
> If we plug data into that we get:
>=20
>   IV =3D (1010****... XOR cipherState)[0:4] | P'[4:12]
>   IV =3D 1010 XOR 0101 | 1111...
>   IV =3D 1111 | 1111... =3D=3D 1111..
>   N =3D 1111... XOR 0101... =3D=3D 1010...
>=20
> and then P and cipherState come out the same as above.
>=20
> Nico
> --


From kwburgi@tycho.ncsc.mil  Fri May 31 13:31:14 2013
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Subject: [kitten] Collected comments on draft-ietf-kitten-aes-cts-hmac-sha2
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I've tried to collect all the comments on =
draft-ietf-kitten-aes-cts-hmac-sha2 in one place (most just copied and =
pasted from earlier mail). If you've made one I missed, or have one to =
make, please let me know. I'm still not sure that there's a plan for 3) =
below.

1) Make no reference to terminology or concepts introduced in the =
simplified profile in RFC 3961. Refer only to RFC 3961 sections 3 and 4. =
Further detailed comments by Sam to be addressed on this.

2) Minimize references to RFC 3962; in general repeating text from RFC =
3962 is probably better than references. Further detailed comments by =
Sam to be addressed on this.

3) New section on random in salts and the issues they raise?=20

4) Include some text in Section 1 that points out there is no =
confounding along with reasons for this design choice.=20

5) Add a solution to the short plaintext problem=20

6) Use cipherState throughout, and just say XOR (instead of + with =
explanation)=

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From: "Cantor, Scott" <cantor.2@osu.edu>
To: Shawn Emery <shawn.emery@oracle.com>, "kitten@ietf.org" <kitten@ietf.org>
Thread-Topic: [kitten] Consensus Calls
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Couple days late, sorry.

> 1. In regards to draft-ietf-kitten-sasl-oauth, RFC 6616, and RFC 6595; do=
 we
> allow for GS2 mechanisms that don't provide mutual authentication?  This
> would entail changing the GS2 specification (RFC 5801) to relax this
> constraint.
>=20
> a. Yes
> b. No
> c. Don't care or need more information

I'm going with (c) specifically in that I'd want to understand the implicat=
ions for existing libraries/code that would have to change. I put a high pr=
emium on avoiding platform lifts. Red Hat 5 and whatever it shipped with wi=
ll be supported but frozen through 2017, to use one egregious example.

-- Scott



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Date: Fri, 31 May 2013 15:45:27 -0500
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From: Nico Williams <nico@cryptonector.com>
To: Kelley Burgin <kwburgi@tycho.ncsc.mil>
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Cc: kitten@ietf.org, Sam Hartman <hartmans-ietf@mit.edu>
Subject: Re: [kitten] Random-IV and short-plaintexts (Re: Comments on draft-ietf-kitten-aes-cts-hmac-sha2-00)
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On Fri, May 31, 2013 at 10:59 AM, Kelley Burgin <kwburgi@tycho.ncsc.mil> wrote:
> This looks great.

Awesome.

> Last comment (I think): The encrypt side considers the case L(P) = c to be short-plaintext, whereas the decrypt side considers it not short ("L(P) > c" vs "L(C') >= c").

Let's call that a typo :)  It should be > in both cases.

> Also, guess C = C' | N[c - PC:PC] in the short-plaintext decrypt should use N'.

Also a typo.

Nico
--
