Hi Ted, Unfortunately, we wont be in Buenos Aires. But I plan to communicate the details to Richard, who may decide to present some of it.
Best, Karthik > On 23 Mar 2016, at 23:54, Ted Hardie <ted.i...@gmail.com> wrote: > > Hi Karthik, > > Thanks for your message. Will you or your co-authors be in Buenos Aires for > the IETF? Would you like to present this work to the working group there, if > so? > > thanks, > > Ted > > On Wed, Mar 23, 2016 at 3:33 PM, Karthik Bhargavan > <karthikeyan.bharga...@inria.fr <mailto:karthikeyan.bharga...@inria.fr>> > wrote: > Dear All, > > Recently, after being asked by Josh Aas, I wrote a formal model of the ACME > protocol > in ProVerif and analyzed it for various properties. I am still in the process > of cleaning > up the model and writing up a proper report, but with the next IETF being so > close, > here’re some early comments that may be useful for the group to discuss. > These notes are inspired by my model of the -01 draft and some of it may be > out of date. > > Summary: > ------------- > > Against a classic symbolic protocol adversary, ACME achieves most of its > security goals. > Notably, it prevents many more attacks than traditional CAs through its use > of client signatures, > and specifically through the strong binding between the client’s account key > and the validated domain. > > However, there are two scenarios of concern that should be studied more > carefully: > (1) if an ACME client supports multiple CAs or ACME servers and one of them > may be malicious or compromised; > (2) if the contact channel is used for account recovery or, in the future, if > an email channel is used for domain validation. > > In both these cases, the protocol as it is currently specified (in -01) is > not strong enough to provide the desired guarantees, > but the good news is that it can be easily strengthened to prevent abuse. > > We describe 3 issues, in increasing order of seriousness. The first two are > closely related and may have been discussed > in the list before. Issue 3 seems to be new and should probably be considered > an attack on the stated goals of the ACME -01 spec. > > Model: > --------- > > Our model consists of four kinds of principals: > - Domain Owners (who can answer domain validation challenges) > - ACME clients (who own account keys) > - ACME servers (who own HTTPS certificates acceptable to ACME clients) > - CAs (who own CA signing certificates) > > An ACME client can talk to any number of ACME servers over three kinds of > channels: > > - HTTPS channels, which are treated as server-authenticated request-response > channels > That is: anybody can send a request but only the server can read it, > only the server can send a response, > and furthermore only the client who sent the request can read > the response. > > - DNS/HTTPS/SNI validation channels, which are treated as > sender-authenticated asynchronous channels > That is: only the domain owner(s) can write on the channel, but anybody > can read it > > - Contact/Email channels, which are treated as receiver-authenticated > asynchronous channels > That is: anybody can write messages on the channel, but only the domain > owner(s) can read it. > > In our model, we can experiment with the compromise of various combinations > of principals. > When a principal is compromised, all the channels they control become > available to the adversary. > For example, if an ACME HTTPS server is malicious or compromised, then its > HTTPS certificate > signing key is known to the adversary, and consequently the ACME channel is > compromised. > > The ACME spec informally assumes that at most one channel is compromised. > In the rest of this email, we primarily consider compromise of the HTTPS > channel > between ACME clients and servers. We assume that the CA signing key and the > honest client’s account key remains secure. > > > Issue 1: No Mutual Authentication > --------------------------------------------- > > The first issue already appears when we model the ACME HTTPS channel. > We would have expected to model this as a mutually-authenticated channel > since the client always signs its messages with the account key. > However, although the client’s signature is tunnelled inside HTTPS, the > signature itself is not “bound” to the HTTPS channel. > > This means that a message from an ACME client C to a server S > can be forwarded by S to a different ACME server S’ (as long as S’ is also > willing > to accept C’s account key). This is a classic “credential forwarding” attack > that is typically mitigated by channel binding. > > For example, ACME could rely on the Token Binding specifications > to securely bind the client signature to the underlying channel: > https://datatracker.ietf.org/wg/tokbind/documents/ > <https://datatracker.ietf.org/wg/tokbind/documents/> > > Alternatively, all ACME messages could include the identity of the ACME server > (this could, for example, be the SNI or server domain name that the ACME > client > checks in the certificate when it connects to the server.) > > Either of these choices would make the HTTPS channel truly > mutually-authenticated, > simplifying a lot of the subsequent analysis. > > Issue 2: Certificate Request not bound to CA > ------------------------------------------------------------ > > Suppose an ACME client C connects to an ACME server S, > and suppose that S’s HTTPS private key is compromised (or that S is malicious, > or a man-in-the-middle has compromised the ACME channel or that the > attacker has obtained a mis-issued certificate for S, or that the attacker > has fooled the client into accepting its certificate). > > Now, the attacker can intercept authorization and certificate requests from C > to S, > and instead forward them to another ACME server S’. If S’ requests domain > validation with a token T, the attacker forwards the token to the client, who > will dutifully place its account key K and token T on its validation channel. > S’ will check this token and accept the authorization and issue a certificate > that the attacker can forward to C. > > This means that C asked for a certificate from S, but instead received a > certificate from S’. > Moreover, it may have paid S for the service, but S’ might have done it for > free. > This request forwarding “attack” can be prevented if C checks the certificate > it gets to make sure it was issued by the expected CA. It can also be > prevented > by channel binding. > > An alternative mitigation would be for ACME to extend the Key Authorization > string to include the CA’s identifier. E.g.: > > key-authz = token || '.' || base64url(JWK_Thumbprint(accountKey)) || ‘.’ || > base64url(server_id) > > Where server_id could be the ACME server’s SNI or certificate-hash. > In other words, the domain validation challenge currently includes the > client’s identity and the server’s challenge, > but it does not include the server’s identity, allowing the challenge > response to be used with multiple servers. > This may well be a privacy feature (?) but if not then adding further context > to the challenge response will add protection > in the multiple CA use case > > > Issue 3: Contact-based Recovery can be Hijacked > ------------------------------------------------------------------- > > The use of sender-authenticated channels in ACME (HTTPS/SNI/DNS) seems to be > relatively secure. > However, more attention needs to be paid to the receiver-authenticated > channels like email, because they are > easy to get wrong. For example, if the ACME server (in some future draft) > uses the website administrator’s email > address to send the domain validation token, a naive implementation of this > kind of challenge would be vulnerable to attack. > > In the -01 specification, the contact channel (typically email) is used for > account recovery > when the ACME client has forgotten its account key. We show how the careless > use of this channel can be vulnerable to attack, and propose a countermeasure. > > Suppose an ACME client C issues an account recovery request for account A > with a new key K to the ACME server S. > A network attacker blocks this request and instead sends his own account > recovery request for account A (pretending to be C) > with his own key K’. The server S will then send C an email asking to click > on a link. > C will think this is a request in response to its own account recovery > request and will click on it. > S will think that C has confirmed account recovery and will transfer the > account A to the attacker’s key K’. > > In the above attack, the attacker did not need to compromise the contact > channel (or for that matter, the ACME channel). > This seems to directly contradict the security considerations in 9.3, unless > I am reading something wrong. > The key observation here is that on receiver-authenticated channels (e.g. > email) the receiver does not get to > bind the token provided by the server with its own account key. Consequently, > we need to add further checks. > > The email sent from S to C should contain a fresh token + C’s new account key > (e.g. within a key-authz field) > Instead of clicking on the link (out-of-band), C should cut and paste the > token into the ACME client which > can first check that the account key provided by the server matches the one > in the ACME client and only > then does it send the token back to the server. > > Alternatively, if we don’t want to change ACME too much, we must require that > the email recipient at C > visually confirms that the account key (thumbprint) provided by the server > matches the one displayed > in the ACME client. > > The attack described here is on account recovery, but a similar attack > appears if we allow email-based > domain validation. A malicious ACME server or man-in-the-middle can then get > certificate issued for C’s > domains with its own public key, without compromising the contact/validation > channel. The mitigation > for that attack would be very similar to the one proposed above. > > Emails with clickable links are *BAD*; we should enhance their security by > linking them better with > the ACME account key. > > > Proposal > --------------- > > I notice that -02 has removed account recovery completely. I would recommend > that we can > include account recovery, by piggybacking on the account roll-over mechanism > and using MACs > instead of bearer tokens sent in emails. > > The proposal that came up in discussions with Richard Barnes is as follows. > > Currently, account roll-over does something like the following: It signs the > roll-over request with the old key, where the request itself contains a > signature of the old key with the new key. > Note that it would be fine to flip the order of these signatures: It could > sign the roll-over request with the new key, where the request itself > contains a signature of the new key with the old key. > > We further observe that account recovery is a form of roll-over where you are > expected to know a secret that has been delivered out-of-band. > So, let’s assume that when the ACME client initiates account recovery, the > server will somehow out-of-band authenticate the user’s request > and issue the user with a MAC key (e.g. it may email a MAC key to the contact > email address, but it would be better advised to ask the user some questions > first.) > > Now, the ACME client can complete the account recovery by sending a message > as follows: It signs the recovery request with a new account key, and the > request itself > contains a MAC of the new key with the recovery MAC key. > > To make this fully uniform with account roll-over, it would also be > attractive to flip the order of signatures in the roll-over request, as > described above, so that the outer > signature is always with the new key, and the inner JWS is either a signature > with the old account key or a MAC with the recovery key. > account key, and the request itself contains a signature of the old key with > the new key. > > > Best, > Karthik > > _______________________________________________ > Acme mailing list > Acme@ietf.org <mailto:Acme@ietf.org> > https://www.ietf.org/mailman/listinfo/acme > <https://www.ietf.org/mailman/listinfo/acme> > >
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