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Versions: 00 01 02 03 04 RFC 3706

                                                    IPSec Working Group
                                                               G. Huang
                                                            S. Beaulieu
   Internet Draft                                          D. Rochefort
   Document: draft-ietf-ipsec-dpd-03.txt            Cisco Systems, Inc.
   Expires: January 2004                                      June 2003
 
 
            A Traffic-Based Method of Detecting Dead IKE Peers
 
 
 Status of this Memo
 
   This document is an Internet-Draft and is in full conformance
   with all provisions of Section 10 of RFC2026.
 
 
   Internet-Drafts are working documents of the Internet Engineering
   Task Force (IETF), its areas, and its working groups.  Note that
   other groups may also distribute working documents as Internet-
   Drafts.
 
   Internet-Drafts are draft documents valid for a maximum of six
   months and may be updated, replaced, or obsoleted by other documents
   at any time.  It is inappropriate to use Internet-Drafts as
   reference material or to cite them other than as "work in progress."
 
   The list of current Internet-Drafts can be accessed at
        http://www.ietf.org/ietf/1id-abstracts.txt
   The list of Internet-Draft Shadow Directories can be accessed at
        http://www.ietf.org/shadow.html.
 
 
 Abstract
 
   This draft describes a method of detecting a dead IKE peer.  The
   method, called Dead Peer Detection (DPD) uses IPSec traffic patterns
   to limit the number of IKE messages sent.  DPD, like other keepalive
   mechanisms, is often necessary to perform IKE peer failover, or to
   reclaim lost resources.
 
 
 Table of Contents
 
   Status of this Memo................................................1
   Abstract...........................................................1
   Table of Contents..................................................1
   1. Introduction....................................................2
   2. Conventions used in this document...............................3
   3. Document Roadmap................................................3
   4. Rationale for Periodic Message Exchange for Proof of Liveliness.3
   5. Keepalives vs. Heartbeats.......................................3
 
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     5.1 Keepalives:..................................................3
     5.2 Heartbeats:..................................................5
   6. DPD Protocol....................................................6
     6.1 DPD Vendor ID................................................6
     6.2 Message Exchanges............................................7
     6.3 NOTIFY(R-U-THERE/R-U-THERE-ACK) Message Format...............7
     6.4 Impetus for DPD Exchange.....................................8
     6.5 Implementation Suggestion....................................8
     6.6 Comparisons..................................................9
   7. Resistance to Replay Attack and False Proof of Liveliness.......9
     7.1 Sequence Number in DPD Messages..............................9
     7.2 Selection and Maintenance of Sequence Numbers...............10
   8. References.....................................................10
   9. Editors' Addresses.............................................11
 
 
 1. Introduction
 
   When two peers communicate with IKE [1] and IPSec [2], the situation
   may arise in which connectivity between the two goes down
   unexpectedly.  This situation can arise because of routing problems,
   one host rebooting, etc., and in such cases, there is often no way
   for IKE and IPSec to identify the loss of peer connectivity.  As
   such, the SAs can remain until their lifetimes naturally expire,
   resulting in a "black hole" situation where packets are tunneled to
   oblivion.   It is often desirable to recognize black holes as soon
   as possible so that an entity can failover to a different peer
   quickly.  Likewise, it is sometimes necessary to detect black holes
   to recover lost resources.
 
   This problem of detecting a dead IKE peer has been addressed by
   proposals that require sending periodic HELLO/ACK messages to prove
   liveliness.  These schemes tend to be unidirectional (a HELLO only)
   or bidirectional (a HELLO/ACK pair).  For the purpose of this draft,
   the term "heartbeat" will refer to a unidirectional message to prove
   liveliness.  Likewise, the term "keepalive" will refer to a
   bidirectional message.
 
   The problem with current heartbeat and keepalive proposals is their
   reliance upon their messages to be sent at regular intervals.  In
   the implementation, this translates into managing some timer to
   service these message intervals.  Similarly, because rapid detection
   of the dead peer is often desired, these messages must be sent with
   some frequency, again translating into considerable overhead for
   message processing.  In implementations and installations where
   managing large numbers of simultaneous IKE sessions is of concern,
   these regular heartbeats/keepalives prove to be infeasible.
 
   To this end, this draft proposes an approach to detect peer
   liveliness without needing to send messages at regular intervals.
 
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   This scheme, called Dead Peer Detection (DPD), relies on IKE Notify
   messages to query the liveliness of an IKE peer.
 
 
 2. Conventions used in this document
 
   The key words "MUST", "MUST NOT", "REQUIRED", "SHALL", "SHALL NOT",
   "SHOULD", "SHOULD NOT", "RECOMMENDED",  "MAY", and "OPTIONAL" in
   this document are to be interpreted as described in RFC-2119 [3].
 
 
 3. Document Roadmap
 
   As mentioned above, there are already proposed solutions to the
   problem of detecting dead peers.  Section 4 elaborates the rationale
   for using an IKE message exchange to query a peer's liveliness.
   Section 5 examines a keepalives-based approach as well as a
   heartbeats-based approach.  Section 6 presents the DPD proposal
   fully, highlighting differences between DPD and the schemes
   presented in Section 5 and emphasizing scalability issues.  Section
   7 examines security issues surrounding replayed messages and false
   liveliness.
 
 4. Rationale for Periodic Message Exchange for Proof of Liveliness
   As the introduction mentioned, it is often necessary to detect a
   peer is unreachable as soon as possible.  IKE provides no way for
   this to occur -- aside from waiting until the rekey period, then
   attempting (and failing the rekey).  This would result in a period
   of loss connectivity lasting the remainder of the lifetime of the
   security association (SA), and in most deployments, this is
   unacceptable.  As such, a method is needed for checking up on a
   peer's state at will.  Different methods have arisen, usually using
   an IKE Notify to query the peer's liveliness.  These methods rely on
   either a bidirectional "keepalive" message exchange (a HELLO
   followed by an ACK), or a unidirectional "heartbeat" message
   exchange (a HELLO only).  The next section considers both of these
   schemes.
 
 
 5. Keepalives vs. Heartbeats
 5.1 Keepalives:
   Consider a keepalives scheme in which peer A and peer B require
   regular acknowledgements of each other's liveliness.  The messages
   are exchanged by means of an authenticated notify payload.  The two
   peers must agree upon the interval at which keepalives are sent,
   meaning that some negotiation is required during Phase 1.  For any
   prompt failover to be possible, the keepalives must also be sent at
   rather frequent intervals -- around 10 seconds or so.  In this
   hypothetical keepalives scenario, peers A and B agree to exchange
   keepalives every 10 seconds.  Essentially, every 10 seconds, one
   peer must send a HELLO to the other.  This HELLO serves as proof of
   liveliness for the sending entity.  In turn, the other peer must
   acknowledge each keepalive HELLO.  If the 10 seconds elapse, and one
 
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   side has not received a HELLO, it will send the HELLO message
   itself, using the peer's ACK as proof of liveliness.  Receipt of
   either a HELLO or ACK causes an entity's keepalive timer to reset.
   Failure to receive an ACK in a certain period of time signals an
   error.  A clarification is presented below:
 
   Scenario 1:
   Peer A's 10-second timer elapses first, and it sends a HELLO to B.
   B responds with an ACK.
 
   Peer A:                              Peer B:
   10 second timer fires;  ------>
   wants to know that B is alive;
   sends HELLO.
                                         Receives HELLO; acknowledges
                                         A's liveliness;
                               <------   resets keepalive timer, sends
                                         ACK.
   Receives ACK as proof of
   B's liveliness; resets timer.
 
   Scenario 2:
   Peer A's 10-second timer elapses first, and it sends a HELLO to B.
   B fails to respond.  A can retransmit, in case its initial HELLO is
   lost.  This situation describes how peer A detects its peer is dead.
 
   Peer A:                              Peer B (dead):
 
   10 second timer fires;  ------X
   wants to know that B is
   alive; sends HELLO.
 
   Retransmission timer    ------X
   expires; initial message
   could have been lost in
   transit; A increments
   error counter and
   sends another HELLO.
 
   . . .
 
   After some number of errors, A assumes B is dead; deletes SAs and
   possibly initiates failover.
 
   An advantage of this scheme is that the party interested in the
   other peer's liveliness begins the message exchange.  In Scenario 1,
   peer A is interested in peer B's liveliness, and peer A consequently
   sends the HELLO.  It is conceivable in such a scheme that peer B
   would never be interested in peer A's liveliness.  In such a case,
   the onus would always lie on peer A to initiate the exchange.
 
 
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 5.2 Heartbeats:
   By contrast, consider a proof-of-liveliness scheme involving
   unidirectional (unacknowledged) messages.  An entity interested in
   its peer's liveliness would rely on the peer itself to send periodic
   messages demonstrating liveliness.  In such a scheme, the message
   exchange might look like this:
 
   Scenario 3:
   Peer A and Peer B are interested in each other's liveliness.  Each
   peer depends on the other to send periodic HELLOs.
 
 
   Peer A:                              Peer B:
   10 second timer fires;  ------>
   sends HELLO.  Timer also
   signals expectation of
   B's HELLO.
                                         Receives HELLO as proof of A's
                                         liveliness.
 
                               <------   10 second timer fires; sends
                                         HELLO.
   Receives HELLO as proof
   of B's liveliness.
 
   Scenario 4:
   Peer A fails to receive HELLO from B and marks the peer dead.  This
   is how an entity detects its peer is dead.
 
   Peer A:                              Peer B (dead):
   10 second timer fires;  ------X
   sends HELLO.  Timer also
   signals expectation of
   B's HELLO.
 
   . . .
 
   Some time passes and A assumes B is dead.
 
   The disadvantage of this scheme is the reliance upon the peer to
   demonstrate liveliness.  To this end, peer B might never be
   interested in peer A's liveliness.  Nonetheless, if A is interested
   B's liveliness, B must be aware of this, and maintain the necessary
   state information to send periodic HELLOs to A.  The disadvantage of
   such a scheme becomes clear in the remote-access scenario.  Consider
   a VPN aggregator that terminates a large number of sessions (on the
   order of 50,000 peers or so).  Each peer requires fairly rapid
   failover, therefore requiring the aggregator to send HELLO packets
   every 10 seconds or so.  Such a scheme simply lacks scalability, as
   the aggregator must send 50,000 messages every few seconds.
 
   In both of these schemes (keepalives and heartbeats), some
   negotiation of message interval must occur, so that each entity can
 
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   know how often its peer expects a HELLO.  This immediately adds a
   degree of complexity.  Similarly, the need to send periodic messages
   (regardless of other IPSec/IKE activity), also increases
   computational overhead to the system.
 
 
 6. DPD Protocol
   DPD addresses the shortcomings of IKE keepalives- and heartbeats-
   schemes by introducing a more reasonable logic governing message
   exchange.  Essentially, keepalives and heartbeats mandate exchange
   of HELLOs at regular intervals.  By contrast, with DPD, each peer's
   DPD state is largely independent of the other's.  A peer is free to
   request proof of liveliness when it needs it -- not at mandated
   intervals.  This asynchronous property of DPD exchanges allows fewer
   messages to be sent, and this is how DPD achieves greater
   scalability.
 
   As an elaboration, consider two DPD peers A and B.  If there is
   ongoing valid IPSec traffic between the two, there is little need
   for proof of liveliness.  The IPSec traffic itself serves as the
   proof of liveliness.  If, on the other hand, a period of time lapses
   during which no packet exchange occurs, the liveliness of each peer
   is questionable.  Knowledge of the peer's liveliness, however, is
   only urgently necessary if there is traffic to be sent.  For
   example, if peer A has some IPSec packets to send after the period
   of idleness, it will need to know if peer B is still alive.  At this
   point, peer A can initiate the DPD exchange.
 
   To this end, each peer may have different requirements for detecting
   proof of liveliness.  Peer A, for example, may require rapid
   failover, whereas peer B's requirements for resource cleanup are
   less urgent.  In DPD, each peer can define its own "worry metric" -
   an interval that defines the urgency of the DPD exchange.
   Continuing the example, peer A might define its DPD interval to be
   10 seconds.  Then, if peer A sends outbound IPSec traffic, but fails
   to receive any inbound traffic for 10 seconds, it can initiate a DPD
   exchange.
 
   Peer B, on the other hand, defines its less urgent DPD interval to
   be 5 minutes.  If the IPSec session is idle for 5 minutes, peer B
   can initiate a DPD exchange the next time it sends IPSec packets to
   A.
 
   It is important to note that the decision about when to initiate a
   DPD exchange is implementation specific.  An implementation might
   even define the DPD messages to be at regular intervals following
   idle periods.  See section 6.5 for more implementation suggestions.
 
 6.1 DPD Vendor ID
   To demonstrate DPD capability, an entity must send the DPD vendor
   ID.  Both peers of an IKE session MUST send the DPD vendor ID before
   DPD exchanges can begin.  The format of the DPD Vendor ID is:
 
 
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                                     1
                0 1 2 3 4 5 6 7 8 9 0 1 2 3 4 5
                +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+
                !                           !M!M!
                !      HASHED_VENDOR_ID     !J!N!
                !                           !R!R!
                +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+
 
   where HASHED_VENDOR_ID = {0xAF, 0xCA, 0xD7, 0x13, 0x68, 0xA1, 0xF1,
   0xC9, 0x6B, 0x86, 0x96, 0xFC, 0x77, 0x57}, and MJR and MNR
   correspond to the current major and minor version of this protocol
   (1 and 0 respectively).  An IKE peer MUST send the Vendor ID if it
   wishes to take part in DPD exchanges.
 
 6.2 Message Exchanges
 
   The DPD exchange is a bidirectional (HELLO/ACK) Notify message.  The
   exchange is defined as:
 
            Sender                                      Responder
           --------                                    -----------
   HDR*, NOTIFY(R-U-THERE), HASH   ------>
 
                                 <------    HDR*, NOTIFY(R-U-THERE-
                                            ACK), HASH
 
   The R-U-THERE message corresponds to a "HELLO" and the R-U-THERE-ACK
   corresponds to an "ACK."  Both messages are simply ISAKMP Notify
   payloads, and as such, this draft defines these two new ISAKMP
   Notify message types:
 
      Notify                      Message Value
      R-U-THERE                   36136
      R-U-THERE-ACK               36137
 
   An entity that has sent the DPD Vendor ID MUST respond to an R-U-
   THERE query.  Furthermore, an entity MUST reject unencrypted R-U-
   THERE and R-U-THERE-ACK messages.
 
 6.3 NOTIFY(R-U-THERE/R-U-THERE-ACK) Message Format
   When sent, the R-U-THERE message MUST take the following form:
 
                       1                   2                   3
   0 1 2 3 4 5 6 7 8 9 0 1 2 3 4 5 6 7 8 9 0 1 2 3 4 5 6 7 8 9 0 1
   +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+
   ! Next Payload  !   RESERVED    !         Payload Length        !
   +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+
   !              Domain of Interpretation  (DOI)                  !
   +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+
   !  Protocol-ID  ! SPI Size = 16 !      Notify Message Type      !
   +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+
   !                                                               !
   ~                Security Parameter Index (SPI)                 ~
 
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   !                                                               !
   +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+
   !                                                               !
   ~                    Notification Data                          ~
   !                                                               !
   +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+
 
   As this message is an ISAKMP NOTIFY, the Next Payload, RESERVED, and
   Payload Length fields should be set accordingly.  The remaining
   fields are set as:
 
   - Domain of Interpretation (4 octets) - SHOULD be set to IPSEC-DOI.
 
   - Protocol ID (1 octet) - MUST be set to the protocol ID for ISAKMP.
 
   - SPI Size (2 octets) - SHOULD be set to sixteen (16), the length of
     two octet-sized ISAKMP cookies.
 
   - Notify Message Type (2 octets) - MUST be set to R-U-THERE
 
   - Security Parameter Index (16 octets) - SHOULD be set to the
     cookies of the Initiator and Responder of the IKE SA (in that
     order)
 
   - Notification Data (4 octets) - MUST be set to the sequence number
     corresponding to this message
 
   The format of the R-U-THERE-ACK message is the same, with the
   exception that the Notify Message Type MUST be set to R-U-THERE-ACK.
   Again, the Notification Data MUST be sent to the sequence number
   corresponding to the received R-U-THERE message.
 
 6.4 Impetus for DPD Exchange
   Again, rather than relying on some negotiated time interval to force
   the exchange of messages, DPD does not mandate the exchange of R-U-
   THERE messages at any time.  Instead, an IKE peer SHOULD send an R-
   U-THERE query to its peer only if it is interested in the liveliness
   of this peer.  To this end, if traffic is regularly exchanged
   between two peers, either peer SHOULD use this traffic as proof of
   liveliness, and both peers SHOULD NOT initiate a DPD exchange.
 
   A peer MUST keep track of the state of a given DPD exchange.  That
   is, once it has sent an R-U-THERE query, it expects an ACK in
   response within some implementation-defined period of time.  An
   implementation SHOULD retransmit R-U-THERE queries when it fails to
   receive an ACK.  After some number of retransmitted messages, an
   implementation SHOULD assume its peer to be unreachable and delete
   IPSec and IKE SAs to the peer.
 
 6.5 Implementation Suggestion
   Since the liveliness of a peer is only questionable when no traffic
   is exchanged, a viable implementation might begin by monitoring
   idleness.  Along these lines, a peer's liveliness is only important
 
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   when there is outbound traffic to be sent.  To this end, an
   implementation can initiate a DPD exchange (i.e., send an R-U-THERE
   message) when there has been some period of idleness, followed by
   the desire to send outbound traffic.  Likewise, an entity can
   initiate a DPD exchange if it has sent outbound IPSec traffic, but
   not received any inbound IPSec packets in response.  A complete DPD
   exchange (i.e., transmission of R-U-THERE and receipt of
   corresponding R-U-THERE-ACK) will serve as proof of liveliness until
   the next idle period.
 
   Again, since DPD does not mandate any interval, this "idle period"
   (or "worry metric") is left as an implementation decision.  It is
   not a negotiated value.
 
 6.6 Comparisons
   The performance benefit that DPD offers over traditional keepalives-
   and heartbeats-schemes comes from the fact that regular messages do
   not need to be sent.  Returning to the examples presented in section
   5.1, a keepalive implementation such as the one presented would
   require one timer to signal when to send a HELLO message and another
   timer to "timeout" the ACK from the peer (this could also be the
   retransmit timer).  Similarly, a heartbeats scheme such as the one
   presented in section 5.2 would need to keep one timer to signal when
   to send a HELLO, as well as another timer to signal the expectation
   of a HELLO from the peer.  By contrast a DPD scheme needs to keep a
   timestamp to keep track of the last received traffic from the peer
   (thus marking beginning of the "idle period").  Once a DPD R-U-THERE
   message has been sent, an implementation need only maintain a timer
   to signal retransmission.  Thus, the need to maintain active timer
   state is reduced, resulting in a scalability improvement (assuming
   maintaining a timestamp is less costly than an active timer).
   Furthermore, since a DPD exchange only occurs if an entity has not
   received traffic recently from its peer, the number of IKE messages
   to be sent and processed is also reduced.  As a consequence, the
   scalability of DPD is much better than keepalives and heartbeats.
 
   DPD maintains the HELLO/ACK model presented by keepalives, as it
   follows that an exchange is initiated only by an entity interested
   in the liveliness of its peer.
 
 
 7. Resistance to Replay Attack and False Proof of Liveliness
 7.1 Sequence Number in DPD Messages
   To guard against message replay attacks and false proof of
   liveliness, a 32-bit sequence number MUST be presented with each R-
   U-THERE message.  A responder to an R-U-THERE message MUST send an
   R-U-THERE-ACK with the same sequence number.  Upon receipt of the R-
   U-THERE-ACK message, the initial sender SHOULD check the validity of
   the sequence number.  The initial sender SHOULD reject the R-U-
   THERE-ACK if the sequence number fails to match the one sent with
   the R-U-THERE message.
 
 
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   Additionally, both the receiver of the R-U-THERE and the R-U-THERE-
   ACK message SHOULD check the validity of the Initiator and Responder
   cookies presented in the SPI field of the payload.
 
 7.2 Selection and Maintenance of Sequence Numbers
   As both DPD peers can initiate a DPD exchange (i.e., both peers can
   send R-U-THERE messages), each peer MUST maintain its own sequence
   number for R-U-THERE messages.  The first R-U-THERE message sent in
   a session MUST be a randomly chosen number.  To prevent rolling past
   overflowing the 32-bit boundary, the high-bit of the sequence number
   initially SHOULD be set to zero.  Subsequent R-U-THERE messages MUST
   increment the sequence number by one.  Sequence numbers MAY reset at
   the expiry of the IKE SA, moving to a newly chosen random number.
   Each entity SHOULD also maintain its peer's R-U-THERE sequence
   number, and an entity SHOULD reject the R-U-THERE message if it
   fails to match the expected sequence number.
 
   Implementations MAY maintain a window of acceptable sequence
   numbers, but this specification makes no assumptions about how this
   is done.  Again, it is an implementation specific detail.
 
 8. Security Considerations
   As the previous section highlighted, DPD uses sequence numbers to
   ensure liveliness.  This section describes the advantages of using
   sequence numbers over random nonces to ensure liveliness.
 
   While sequence numbers do require entities to keep per-peer state,
   they also provide an added method of protection in certain replay
   attacks.  Consider a case where peer A sends peer B a valid DPD R-U-
   THERE message.  An attacker C can intercept this message and flood B
   with multiple copies of the messages.  B will have to decrypt and
   process each packet (regardless of whether sequence numbers or
   nonces are in use).  With sequence numbers B can detect that the
   packets are replayed: the sequence numbers in these replayed packets
   will not match the incremented sequence number that B expects to
   receive from A.  This prevents B from needing to build, encrypt, and
   send ACKs.  By contrast, if the DPD protocol used nonces, it would
   provide no way for B to detect that the messages are replayed
   (unless B maintained a list of recently received nonces).
 
   Another benefit of sequence numbers is that it adds an extra
   assurance of the peer's liveliness.  As long as a receiver verifies
   the validity of a DPD R-U-THERE message (by verifying its
   incremented sequence number), then the receiver can be assured of
   the peer's liveliness by the very fact that the sender initiated the
   query.  Nonces, by contrast, cannot provide this assurance.
 
 9. IANA Considerations
   There is no IANA action required for this draft.  DPD uses notify
   numbers from the private range.
 
 
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 10. References
   1  RFC 2409 Harkins, D. and Carrel, D., "The Internet Key Exchange
      (IKE)," November 1998.
 
   2  RFC 2401 Kent, S. and Atkinson, R., "Security Architecture for
      the Internet Protocol," November 1998.
 
   3  RFC 2119 Bradner, S., "Key words for use in RFCs to Indicate
      Requirement Levels," BCP 14, RFC 2119, March 1997.
 
 10. Editors' Addresses
 
   Geoffrey Huang
   Cisco Systems, Inc.
   170 West Tasman Drive
   San Jose, CA 95134
   Phone: (408) 525-5354
   Email: ghuang@cisco.com
 
   Stephane Beaulieu
   Cisco Systems, Inc.
   2000 Innovation Drive
   Kanata, ON
   Canada, K2K 3E8
   Phone: (613) 271-3678
   Email: stephane@cisco.com
 
   Dany Rochefort
   Cisco Systems, Inc.
   124 Grove Street, Suite 205
   Franklin, MA 02038
   Phone: (508) 553-6136
   Email: danyr@cisco.com
 
   The IPsec working group can be contacted through the chairs:
 
   Barbara Fraser
   byfraser@cisco.com
   Cisco Systems, Inc.
 
   Ted T'so
   tytso@mit.edu
   Massachusetts Institute of Technology
 
 
 
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