Network Working Group D. Harkins
Internet-Draft Aruba Networks
Intended status: Experimental March 26, 2012
Expires: September 27, 2012
Secure PSK Authentication for IKE
draft-harkins-ipsecme-spsk-auth-08
Abstract
This memo describes a secure pre-shared key authentication method for
IKE. It is resistant to dictionary attack and retains security even
when used with weak pre-shared keys.
Status of this Memo
This Internet-Draft is submitted in full conformance with the
provisions of BCP 78 and BCP 79.
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This Internet-Draft will expire on September 27, 2012.
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Table of Contents
1. Introduction . . . . . . . . . . . . . . . . . . . . . . . . . 3
1.1. Keyword Definitions . . . . . . . . . . . . . . . . . . . 3
2. Usage Scenarios . . . . . . . . . . . . . . . . . . . . . . . 3
3. Terms and Notation . . . . . . . . . . . . . . . . . . . . . . 4
4. Discrete Logarithm Cryptography . . . . . . . . . . . . . . . 5
4.1. Elliptic Curve Cryptography (ECP) Groups . . . . . . . . . 5
4.2. Finite Field Cryptography (MODP) Groups . . . . . . . . . 7
5. Random Numbers . . . . . . . . . . . . . . . . . . . . . . . . 7
6. Using Passwords and Raw Keys For Authentication . . . . . . . 8
7. Assumptions . . . . . . . . . . . . . . . . . . . . . . . . . 9
8. Secure PSK Authentication Message Exchange . . . . . . . . . . 9
8.1. Negotiation of Secure PSK Authentication . . . . . . . . . 10
8.2. Fixing the Secret Element, SKE . . . . . . . . . . . . . . 10
8.2.1. ECP Operation to Select SKE . . . . . . . . . . . . . 11
8.2.2. MODP Operation to Select SKE . . . . . . . . . . . . . 13
8.3. Encoding and Decoding of Group Elements and Scalars . . . 14
8.3.1. Encoding and Decoding of Scalars . . . . . . . . . . . 14
8.3.2. Encoding and Decoding of ECP Elements . . . . . . . . 15
8.3.3. Encoding and Decoding of MODP Elements . . . . . . . . 15
8.4. Message Generation and Processing . . . . . . . . . . . . 15
8.4.1. Generation of a Commit . . . . . . . . . . . . . . . . 15
8.4.2. Processing of a Commit . . . . . . . . . . . . . . . . 16
8.4.2.1. Validation of an ECP Element . . . . . . . . . . . 16
8.4.2.2. Validation of a MODP Element . . . . . . . . . . . 16
8.4.2.3. Commit Processing Steps . . . . . . . . . . . . . 16
8.4.3. Authentication of the Exchange . . . . . . . . . . . . 17
8.5. Payload Format . . . . . . . . . . . . . . . . . . . . . . 18
8.5.1. Commit Payload . . . . . . . . . . . . . . . . . . . . 18
8.6. IKEv2 Messaging . . . . . . . . . . . . . . . . . . . . . 18
9. IANA Considerations . . . . . . . . . . . . . . . . . . . . . 19
10. Security Considerations . . . . . . . . . . . . . . . . . . . 20
11. Acknowledgements . . . . . . . . . . . . . . . . . . . . . . . 22
12. References . . . . . . . . . . . . . . . . . . . . . . . . . . 22
12.1. Normative References . . . . . . . . . . . . . . . . . . . 22
12.2. Informative References . . . . . . . . . . . . . . . . . . 23
Author's Address . . . . . . . . . . . . . . . . . . . . . . . . . 23
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1. Introduction
[RFC5996] allows for authentication of the IKE peers using a pre-
shared key. This exchange, though, is susceptible to dictionary
attack and is therefore insecure when used with weak pre-shared keys,
such as human-memorizable passwords. To address the security issue,
[RFC5996] recommends that the pre-shared key used for authentication
"contain as much unpredictability as the strongest key being
negotiated". That means any non-hexidecimal key would require over
100 characters to provide enough strength to generate a 128-bit key
suitable for AES. This is an unrealistic requirement because humans
have a hard time entering a string over 20 characters without error.
Consequently, pre-shared key authentication in [RFC5996] is used
insecurely today.
A pre-shared key authentication method built on top of a zero-
knowledge proof will provide resistance to dictionary attack and
still allow for security when used with weak pre-shared keys, such as
user-chosen passwords. Such an authentication method is described in
this memo.
Resistance to dictionary attack is achieved when an adversary gets
one, and only one, guess at the secret per active attack (see for
example, [BM92], [BMP00] and [BPR00]). Another way of putting this
is that any advantage the adversary can realize is through
interaction and not through computation. This is demonstrably
different than the technique from [RFC5996] of using a large, random
number as the pre-shared key. That can only make a dictionary attack
less likely to succeed, it does not prevent a dictionary attack.
And, as [RFC5996] notes, it is completely insecure when used with
weak keys like user-generated passwords.
1.1. Keyword Definitions
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 [RFC2119].
2. Usage Scenarios
[RFC5996] describes usage scenarios for IKEv2. These are:
1. "Security Gateway to Security Gateway Tunnel": the endpoints of
the IKE (and IPsec) communication are network nodes that protect
traffic on behalf of connected networks. Protected traffic is
between devices on the respective protected networks.
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2. "Endpoint-to-Endpoint Transport": the endpoints of the IKE (and
IPsec) communication are hosts according to [RFC4301]. Protected
traffic is between the two endpoints.
3. "Endpoint to Security Gateway Tunnel": one endpoint connects to a
protected network through a network node. The endpoints of the
IKE (and IPsec) communication are the endpoint and network node,
but the protected traffic is between the endpoint and another
device on the protected network behind the node.
The authentication and key exchange described in this memo is
suitable for all the usage scenarios described in [RFC5996]. In the
"Security Gateway to Security Gateway Tunnel" scenario and the
"Endpoint-to-Endpoint Transport" scenario it provides a secure method
of authentication without requiring a certificate. For the "Endpoint
to Security Gateway Tunnel" scenario it provides for secure username+
password authentication that is popular in remote access VPN
situations.
3. Terms and Notation
The following terms and notation are used in this memo:
PSK
A shared, secret and potentially low-entropy word, phrase, code
or key used as a credential to mutually authenticate the peers.
a = prf(b, c)
The string "b" and "c" are given to a pseudo-random function to
produce a fixed-length output "a".
a | b
denotes concatenation of string "a" with string "b".
[a]b
indicates a string consisting of the single bit "a" repeated "b"
times.
len(a)
indicates the length in bits of the string "a".
LSB(a)
returns the least-significant bit of the bitstring "a".
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element
one member of a finite cyclic group.
scalar
a quantity that can multiply an element.
The convention for this memo to represent an element in a finite
cyclic group is to use an upper-case letter or acronym, while a
scalar is indicated with a lower-case letter or acronym.
4. Discrete Logarithm Cryptography
This protocol uses Discrete Logarithm Cryptography to achieve
authentication. Each party to the exchange derives ephemeral public
and private keys with respect to a particular set of domain
parameters (referred to here as a "group"). Groups can be either
based on finite field cryptography (MODP groups) or elliptic curve
cryptography (ECP groups).
This protocol uses the same group as the IKE exchange in which it is
being used for authentication, with the exception of characteristic-
two elliptic curve groups (EC2N). Use of such groups is undefined
for this authentication method and an IKE exchange that negotiates
one of these groups MUST NOT use this method of authentication.
For each group the following operations are defined:
o "scalar operation"-- takes a scalar and an element in the group
to produce another element-- Z = scalar-op(x, Y).
o "element operation"-- takes two elements in the group to produce
a third-- Z = element-op(X, Y).
o "inverse operation"-- takes an element and returns another
element such that the element operation on the two produces the
identity element of the group-- Y = inverse(X).
4.1. Elliptic Curve Cryptography (ECP) Groups
The key exchange defined in this memo uses fundamental algorithms of
ECP groups as described in [RFC6090].
Domain parameters for ECP elliptic curves used for secure pre-shared
key-based authentication include:
o A prime, p, determining a prime field GF(p). The cryptographic
group will be a subgroup of the full elliptic curve group which
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consists of points on an elliptic curve-- elements from GF(p) that
satisfy the curve's equation-- together with the "point at
infinity" (denoted here as "0") that serves as the identity
element.
o Elements a and b from GF(p) that define the curve's equation. The
point (x,y) is on the elliptic curve if and only if y^2 = x^3 +
a*x + b.
o A prime, r, which is the order of G, and thus is also the size of
the cryptographic subgroup that is generated by G.
The scalar operation is multiplication of a point on the curve by
itself a number of times. The point Y is multiplied x-times to
produce another point Z:
Z = scalar-op(x, Y) = x*Y
The element operation is addition of two points on the curve. Points
X and Y are summed to produce another point Z:
Z = element-op(X, Y) = X + Y
The inverse function is defined such that the sum of an element and
its inverse is "0", the point-at-infinity of an elliptic curve group:
Q + inverse(Q) = "0"
Elliptic curve groups require a mapping function, q = F(Q), to
convert a group element to an integer. The mapping function used in
this memo returns the x-coordinate of the point it is passed.
scalar-op(x, Y) can be viewed as x iterations of element-op() by
defining:
Y = scalar-op(1, Y)
Y = scalar-op(x, Y) = element-op(Y, scalar-op(x-1, Y)), for x > 1
A definition of how to add two points on an elliptic curve (i.e.
element-op(X, Y)) can be found in [RFC6090].
Note: There is another ECP domain parameter, a co-factor, h, that is
defined by the requirement that the size of the full elliptic curve
group (including "0") be the product of h and r. ECP groups used for
secure pre-shared key-based authentication MUST have a co-factor of
one (1). At the time of publication of this memo, all ECP groups in
[IKEV2-IANA] had a co-factor of one (1).
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4.2. Finite Field Cryptography (MODP) Groups
Domain parameters for MODP groups used for secure pre-shared key-
based authentication include:
o A prime, p, determining a prime field GF(p), the integers modulo
p.
o A prime, r, which is the multiplicative order of G, and thus also
the size of the cryptographic subgroup of GF(p)* that is generated
by G.
The scalar operation is exponentiation of a generator modulo a prime.
An element Y is taken to the x-th power modulo the prime returning
another element, Z:
Z = scalar-op(x, Y) = Y^x mod p
The element operation is modular multiplication. Two elements, X and
Y, are multiplied modulo the prime returning another element, Z:
Z = element-op(X, Y) = (X * Y) mod p
The inverse function for a MODP group is defined such that the
product of an element and its inverse modulo the group prime equals
one (1). In other words,
(Q * inverse(Q)) mod p = 1
Unlike ECP groups, MODP groups do not require a mapping function to
convert an element into an integer. But for the purposes of notation
in protocol definition, the function F, when used below, shall just
return the value that was passed to it-- i.e. F(i) = i.
Some MODP groups in [IKEV2-IANA] are based on safe primes and the
order is not included in the group's domain parameter set. In this
case only, the order, r, MUST be computed as the prime minus one
divided by two-- (p-1)/2. If an order is included in the group's
domain parameter set that value MUST be used in this exchange when an
order is called for. If a MODP group does not include an order in
its domain parameter set and is not based on a safe prime it MUST NOT
be used with this exchange.
5. Random Numbers
As with IKE itself, the security of the secure pre-shared key
authentication method relies upon each participant in the protocol
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producing quality secret random numbers. A poor random number chosen
by either side in a single exchange can compromise the shared secret
from that exchange and open up the possibility of dictionary attack.
Producing quality random numbers without specialized hardware entails
using a cryptographic mixing function (like a strong hash function)
to mix entropy from multiple, uncorrelated sources of information and
events. A very good discussion of this can be found in [RFC4086].
6. Using Passwords and Raw Keys For Authentication
The PSK used as an authentication credential with this protocol can
be either a character-based password or passphrase, or it could be a
binary or hexidecimal string. Regardless though, this protocol
requires both the Initiator and Responder to have identical binary
representations of the shared credential.
If the PSK is a character-based password or passphrase, there are two
types of pre-preprocessing that SHALL be employed to convert the
password or passphrase into a hexidecimal string suitable for use
with Secure PSK authentication. If a PSK is already a hexidecimal or
binary string it can be used directly as the shared credential
without any pre-processing.
The first step of pre-processing is to remove ambiguities that may
arise due to internationalization. Each character-based password or
passphrase MUST be pre-processed to remove that ambiguity by
processing the character-based password or passphrase according to
the rules of the [RFC4013] profile of [RFC3454]. The password or
passphrase SHALL be considered a "stored string" per [RFC3454] and
unassigned code points are therefore prohibited. The output SHALL be
the binary representation of the processed UTF-8 character string.
Prohibited output and unassigned codepoints encountered in SASLprep
pre-processing SHALL cause a failure of pre-processing and the output
SHALL NOT be used with Secure Password Authentication.
The next pre-processing step for character-based passwords or
passphrases is to effectively obfuscate the string. This is done in
an attempt to reduce exposure of stored passwords in the event of
server compromise, or compromise of a server's database of stored
passwords. The step involves taking the output of the [RFC4013]
profile of [RFC3454] and passing it, as the key, with the ASCII
string "IKE Secure PSK Authentication", as the data, to HMAC-
SHA256(). The output of this obfuscation step SHALL become the
shared credential used with Secure PSK Authentication.
Note: Passwords tend to be shared for multiple purposes and
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compromise of a server or database of stored plaintext passwords can
be used, in that event, to mount multiple attacks. The obfuscation
step is merely to hide the password in the event of server compromise
or compromise of the database of stored passwords. Advances in
distributed computing power have diminished the effectiveness of
performing multiple prf iterations as a technique to prevent
dictionary attacks, so no such behavior is proscribed here. Mutually
consenting implementations can agree to use a different password
obfuscation method, the one described here is for interoperability
purposes only.
If a device stores passwords for use at a later time it SHOULD pre-
process the password prior to storage. If a user enters a password
into a device at authentication time it MUST be pre-processed upon
entry and prior to use with Secure PSK Authentication.
7. Assumptions
The security of the protocol relies on certain assumptions. They
are:
1. The pseudo-random function, prf, defined in [RFC5996], acts as an
"extractor" (see [RFC5869]) by distilling the entropy from a
secret input into a short, fixed, string. The output of prf is
indistinguishable from a random source.
2. The discrete logarithm problem for the chosen finite cyclic group
is hard. That is, given G, p and Y = G^x mod p it is
computationally infeasible to determine x. Similarly for an
elliptic curve group given the curve definition, a generator G,
and Y = x * G it is computationally infeasible to determine x.
3. The pre-shared key is drawn from a finite pool of potential keys.
Each possible key in the pool has equal probability of being the
shared key. All potential adversaries have access to this pool
of keys.
8. Secure PSK Authentication Message Exchange
The key exchange described in this memo is based on the "Dragonfly"
key exchange which has also been proposed in 802.11 wireless networks
(see [SAE]) and as an EAP method (see [RFC5931]). "Dragonfly" is
patent-free and royalty-free. It SHALL use of the same pseudo-random
function (prf) and the same Diffie-Hellman group that are negotiated
for use in the IKE exchange that "dragonfly" is authenticating.
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A pseudo-random function which uses a block cipher is NOT RECOMMENDED
for use with Secure PSK Authentication due to its poor job operating
as an "extractor" (see Section 7). Pseudo-random functions based on
hash functions using the HMAC construct from [RFC2104] SHOULD be
used.
To perform secure pre-shared key authentication each side must
generate a shared and secret element in the chosen group based on the
pre-shared key. This element, called the Secret Key Element, or SKE,
is then used in the "Dragonfly" authentication and key exchange
protocol. "Dragonfly" consists of each side exchanging a "Commit"
payload and then proving knowledge of the resulting shared secret.
The "Commit" payload contributes ephemeral information to the
exchange and binds the sender to a single value of the pre-shared key
from the pool of potential pre-shared keys. An authentication
payload (AUTH) proves that the pre-shared key is known and completes
the zero-knowledge proof.
8.1. Negotiation of Secure PSK Authentication
The Initiator indicates its desire to use Secure PSK Authentication,
by adding a Notify payload of type SECURE_PASSWORD_METHODS (see
[RFC6467]) to the first message of the IKE_SA_INIT exchange and by
including TBD in the notification data field of the Notify payload,
indicating SPSK Authentication.
The Responder indicates its acceptance to perform Secure PSK
Authentication, by adding a Notify payload of type
SECURE_PASSWORD_METHODS to its response in the IKE_SA_INIT exchange
and by adding the sole value of TBD to the notification data field of
the Notify payload.
If the Responder does not include a Notify payload of type
SECURE_PASSWORD_METHODS in its IKE_SA_INIT response the Initiator
MUST terminate the exchange, it MUST NOT fall back to the PSK
authentication method of [RFC5996]. If the Initiator only indicated
its support for Secure PSK Authentication (i.e. if the Notify data
field only contained TBD) and the Responder replies with a Notify
payload of type SECURE_PASSWORD_METHODS and a different value in the
Notify data field, the Initiator MUST terminate the exchange.
8.2. Fixing the Secret Element, SKE
The method of fixing SKE depends on the type of group, either MODP or
ECP. The function "prf+" from [RFC5996] is used as a key derivation
function.
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Fixing SKE involves an iterative hunting-and-pecking technique using
the prime from the negotiated group's domain parameter set and an
ECP- or MODP-specific operation depending on the negotiated group.
This technique requires the pre-shared key to be a binary string,
therefore any pre-processing transformation (see Section 6) MUST be
performed on the pre-shared key prior to fixing SKE.
To thwart side channel attacks which attempt to determine the number
of iterations of the "hunting-and-pecking" loop that are used to find
SKE for a given password, a security parameter, k, is used to ensure
that at least k iterations are always performed.
Prior to beginning the hunting-and-pecking loop, an 8-bit counter is
set to the value one (1). Then the loop begins. First, the pseudo-
random function is used to generate a secret seed using the counter,
the pre-shared key, and two nonces (without the fixed headers)
exchanged by the Initiator and the Responder (see Section 8.6):
ske-seed = prf(Ni | Nr, psk | counter)
Then, the ske-seed is expanded using prf+ to create an ske-value:
ske-value = prf+(ske-seed, "IKE SKE Hunting And Pecking")
where len(ske-value) is the same as len(p), the length of the prime
from the domain parameter set of the negotiated group.
If the ske-seed is greater than or equal to the prime, p, the counter
is incremented and a new ske-seed is generated and the hunting-and-
pecking continues. If ske-seed is less than the prime, p, it is
passed to the group-specific operation to select the SKE or fail. If
the group-specific operation fails, the counter is incremented, a new
ske-seed is generated and the hunting-and-pecking continues. This
process continues until the group-specific operation returns the
password element. After the password element has been chosen, a
random number is used in place of the password in the ske-seed
calculation and the hunting-and-pecking continues until the counter
is greater than the security parameter, k.
8.2.1. ECP Operation to Select SKE
The group-specific operation for ECP groups uses ske-value, ske-seed
and the equation of the curve to produce SKE. First ske-value is
used directly as the x-coordinate, x, with the equation of the
elliptic curve, with parameters a and b from the domain parameter set
of the curve, to solve for a y-coordinate, y.
Note: A method of checking whether a solution to the equation of the
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elliptic curve is to see whether the legendre symbol of (x^3 + ax +
b) equals one (1). If it does then a solution exists, if it does not
then there is no solution.
If there is no solution to the equation of the elliptic curve then
the operation fails, the counter is incremented, a new ske-value and
ske-seed is selected and the hunting-and-pecking continues. If there
is a solution then, y is calculated as the square root of (x^3 + ax +
b) using the equation of the elliptic curve. In this case an
ambiguity exists as there are technically two solutions to the
equation, and ske-seed is used to unambiguously select one of them.
If the low-order bit of ske-seed is equal to the low-order bit of y
then a candidate SKE is defined as the point (x,y); if the low-order
bit of ske-seed differs from the low-order bit of y then a candidate
SKE is defined as the point (x, p-y) where p is the prime from the
negotiated group's domain parameter set. The candidate SKE becomes
the SKE and the ECP-specific operation completes successfully.
Algorithmically, the process looks like this:
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found = 0
counter = 1
v = psk
do {
ske-seed = prf(Ni | Nr, v | counter)
ske-value = prf+(ske-seed, "IKE SKE Hunting And Pecking")
if (ske-value < p)
then
x = ske-value
if ( (y = sqrt(x^3 + ax + b)) != FAIL)
then
if (found == 0)
then
if (LSB(y) == LSB(ske-seed))
then
SKE = (x,y)
else
SKE = (x, p-y)
fi
found = 1
v = random()
fi
fi
fi
counter = counter + 1
} while ((found == 0) || (counter <= k))
where FAIL indicates that there is no solution to sqrt(x^3 + ax + b).
Figure 1: Fixing SKE for ECP Groups
Note: For ECP groups, the probability that more than "n" iterations
of the "hunting-and-pecking" loop are required to find SKE is roughly
(1-(r/2p))^n which rapidly approaches zero (0) as "n" increases.
8.2.2. MODP Operation to Select SKE
The group-specific operation for MODP groups takes ske-value, and the
prime, p, and order, r, from the group's domain parameter set to
directly produce a candidate SKE by exponentiating the ske-value to
the value ((p-1)/r) modulo the prime. If the candidate SKE is
greater than one (1) the candidate SKE becomes the SKE and the MODP-
specific operation completes successfully. Otherwise, the MODP-
specific operation fails (and the hunting-and-pecking continues).
Algorithmically, the process looks like this:
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found = 0
counter = 1
v = psk
do {
ske-seed = prf(Ni | Nr, v | counter)
ske-value = prf+(ske-seed, "IKE SKE Hunting And Pecking")
if (ske-value < p)
then
ELE = ske-value ^ ((p-1)/r) mod p
if (ELE > 1)
then
if (found == 0)
SKE = ELE
found = 1
v = random()
fi
fi
fi
counter = counter + 1
} while ((found == 0) || (counter <= k))
Figure 2: Fixing SKE for MODP Groups
Note: For MODP groups, the probability that more than "n" iterations
of the "hunting-and-pecking" loop are required to find SKE is roughly
((m-p/p)^n, where m is the largest unsigned number that can be
expressed in len(p) bits, which rapidly approaches zero (0) as "n"
increases.
8.3. Encoding and Decoding of Group Elements and Scalars
The payloads used in the secure pre-shared key authentication method
contain elements from the negotiated group and scalar values. To
ensure interoperability, scalars and field elements MUST be
represented in payloads in accordance with the requirements in this
section.
8.3.1. Encoding and Decoding of Scalars
Scalars MUST be represented (in binary form) as unsigned integers
that are strictly less than r, the order of the generator of the
agreed-upon cryptographic group. The binary representation of each
scalar MUST have a bit length equal to the bit length of the binary
representation of r. This requirement is enforced, if necessary, by
prepending the binary representation of the integer with zeros until
the required length is achieved.
Scalars in the form of unsigned integers are converted into octet-
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strings and back again using the technique described in [RFC6090].
8.3.2. Encoding and Decoding of ECP Elements
Elements in ECP groups are points on the negotiated elliptic curve.
Each such element MUST be represented by the concatenation of two
components, an x-coordinate and a y-coordinate.
Each of the two components, the x-coordinate and the y-coordinate,
MUST be represented (in binary form) as an unsigned integer that is
strictly less than the prime, p, from the group's domain parameter
set. The binary representation of each component MUST have a bit
length equal to the bit length of the binary representation of p.
This length requirement is enforced, if necessary, by prepending the
binary representation of the integer with zeros until the required
length is achieved.
The unsigned integers that represent the coordinates of the point are
converted into octet-strings and back again using the technique
described in [RFC6090].
Since the field element is represented in a payload by the
x-coordinate followed by the y-coordinate it follows, then, that the
length of the element in the payload MUST be twice the bit length of
p.
8.3.3. Encoding and Decoding of MODP Elements
Elements in MODP groups MUST be represented (in binary form) as
unsigned integers that are strictly less than the prime, p, from the
group's domain parameter set. The binary representation of each
group element MUST have a bit length equal to the bit length of the
binary representation of p. This length requirement is enforced, if
necessary, by prepending the binary representation of the interger
with zeros until the required length is achieved.
The unsigned integer that represents a MODP element is converted into
an octet-string and back using the technique described in [RFC6090].
8.4. Message Generation and Processing
8.4.1. Generation of a Commit
Before a Commit can be generated, the SKE must be fixed using the
process described in Section 8.2.
A Commit has two components, a scalar and an Element. To generate a
Commit, two random numbers, a "private" value and a "mask" value, are
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generated (see Section 5). Their sum modulo the order of the group,
r, becomes the scalar component:
scalar = (private + mask) mod r
If the scalar is not greater than one (1), the private and mask
values MUST be thrown away and new values randomly generated. If the
scalar is greater than one (1), the inverse of the scalar operation
with the mask and SKE becomes the Element component.
Element = inverse(scalar-op(mask, SKE))
The Commit payload consists of the scalar followed by the Element and
the scalar and Element are encoded in the Commit payload according to
Section 8.3.
8.4.2. Processing of a Commit
Upon receipt of a peer's Commit the scalar and element MUST be
validated. The processing of an element depends on the type, either
an ECP element or a MODP element.
8.4.2.1. Validation of an ECP Element
Validating a received ECP Element involves: 1) checking whether the
two coordinates, x and y, are both greater than zero (0) and less
than the prime defining the underlying field; and 2) checking whether
the x- and y-coordinates satisfy the equation of the curve (that is,
that they produce a valid point on the curve that is not "0"). If
either of these conditions are not met the received Element is
invalid, otherwise the received Element is valid.
8.4.2.2. Validation of a MODP Element
A received MODP Element is valid if: 1) it is between one (1) and the
prime, p, exclusive; and 2) if modular exponentiation of the Element
by the group order, r, equals one (1). If either of these conditions
are not true the received Element is invalid, otherwise the received
Element is valid..
8.4.2.3. Commit Processing Steps
Commit validation is accomplished by the following steps:
1. The length of the Commit payload is checked against its
anticipated length (the anticipated length of the scalar plus the
anticipated length of the element, for the negotiated group). If
it is incorrect, the Commit is invalidated, otherwise processing
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continues.
2. The peer's scalar is extracted from the Commit payload according
to Section 8.3.1 and checked to ensure it is between one (1) and
r, the order of the negotiated group, exclusive. If it is not,
the Commit is invalidated, otherwise processing continues.
3. The peer's Element is extracted from the Commit payload according
to Section 8.3.2 and checked in a manner that depends on the type
of group negotiated. If the group is ECP the element is
validated according to Section 8.4.2.1, if the group is MODP the
element is validated according to Section 8.4.2.2. If the
Element is not valid then the Commit is invalidated, otherwise
the Commit is validated.
4. The Initiator of the IKE exchange has an added requirement to
verify that the received element and scalar from the Commit
payload differ from the element and scalar sent to the Responder.
If they are identical, it signifies a reflection attack and the
Commit is invalidated.
If the Commit is invalidated the payload MUST be discarded and the
IKE exchange aborted.
8.4.3. Authentication of the Exchange
After a Commit has been generated and a peer's Commit has been
processed a shared secret used to authenticate the peer is derived.
Using SKE, the "private" value generated as part of Commit
generation, and the peer's scalar and Element from its Commit, named
here peer-scalar and peer-element, respectively, a preliminary shared
secret, skey, is generated as:
skey = F(scalar-op(private,
element-op(peer-element,
scalar-op(peer-scalar, SKE))))
For the purposes of subsequent computation, the bit length of skey
SHALL be equal to the bit length of the prime, p, used in either a
MODP or ECP group. This bit length SHALL be enforced, if necessary,
by prepending zeros to the value until the required length is
achieved.
A shared secret, ss, is then computed from skey and the nonces
exchanged by the Initiator (Ni) and Responder (Nr) (without the fixed
headers) using prf():
ss = prf(Ni | Nr, skey | "Secure PSK Authentication in IKE")
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The shared secret, ss, is used in an AUTH authentication payload to
prove possession of the shared secret, and therefore knowledge of the
pre-shared key.
8.5. Payload Format
8.5.1. Commit Payload
[RFC6467] defines a Generic Secure Password Method (GSPM) payload
which is used to convey information that is specific to a particular
secure password method. This memo uses the GSPM payload as a "Commit
Payload" to contain the Scalar and Element used in the SPSK exchange:
The Commit Payload is defined as follows:
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 !C! RESERVED ! Payload Length !
+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+
| |
+ Scalar ~
| |
~ +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+
| | |
+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+ ~
| |
~ Element ~
| |
+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+
The Scalar and Element SHALL be encoded in the Commit payload
according to Section 8.3.
8.6. IKEv2 Messaging
SPSK authentication modifies the IKE_AUTH exchange by adding one
additional round trip to exchange Commit payloads to perform the
Secure PSK Authentication exchange, and by changing the calculation
of the AUTH payload data to bind the IKEv2 exchange to the outcome of
the Secure PSK Authentication exchange (see Figure 3).
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Initiator Responder
----------- -----------
IKE_SA_INIT:
HDR, SAi1, KEi, Ni,
N(SPM-SPSK) -->
<-- HDR, SAr1, KEr, Nr,
N(SPM-SPSK)
IKE_AUTH:
HDR, SK {IDi, COMi, [IDr,]
SAi2, TSi, TSr} -->
<-- HDR, SK {IDr, COMr}
HDR, SK {AUTHi} -->
<-- HDR, SK {AUTHr, SAr2, TSi, TSr}
where N(SPM-SPSK) indicates the Secure Password Methods Notify
payloads used to negotiate the use of SPSK authentication (see
Section 8.1), COMi and AUTHi are the Commit payload and AUTH payload,
respectively, sent by the Initiator and COMr and AUTHr are the Commit
payload and AUTH payload, respectively, sent by the Responder.
Figure 3: Secure PSK in IKEv2
The AUTH payloads when doing SPSK authentication SHALL be computed as
AUTHi = prf(ss, | COMi | COMr)
AUTHr = prf(ss, | COMr | COMi)
Where "ss" is the shared secret derived in Section 8.4.3, COMi and
COMr are the entire Commit payloads (including the fixed headers)
sent by the Initiator and Responder, respectively, and
and are defined in
[RFC5996]. The Authentication Method indicated in both AUTH payloads
SHALL be "Generic Secure Password Authentication Method", value 12,
from [IKEV2-IANA].
9. IANA Considerations
IANA SHALL assign a value for "Secure PSK Authentication", replacing
TBD above, from the Secure Password Authentication Method registry in
[IKEV2-IANA] with the method name of "Secure PSK Authentication".
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10. Security Considerations
Both the Initiator and Responder obtain a shared secret, "ss" (see
Section 8.4.3) based on a secret group element and their own private
values contributed to the exchange. If they do not share the same
pre-shared key they will be unable to derive the same secret group
element and if they do not share the same secret group element they
will be unable to derive the same shared secret.
Resistance to dictionary attack means that the adversary must launch
an active attack to make a single guess at the pre-shared key. If
the size of the pool from which the key was extracted was D, and each
key in the pool has an equal probability of being chosen, then the
probability of success after a single guess is 1/D. After X guesses,
and removal of failed guesses from the pool of possible keys, the
probability becomes 1/(D-X). As X grows so does the probability of
success. Therefore it is possible for an adversary to determine the
pre-shared key through repeated brute-force, active, guessing
attacks. This authentication method does not presume to be secure
against this and implementations SHOULD ensure the size of D is
sufficiently large to prevent this attack. Implementations SHOULD
also take countermeasures, for instance refusing authentication
attempts for a certain amount of time, after the number of failed
authentication attempts reaches a certain threshold. No such
threshold or amount of time is recommended in this memo.
An active attacker can impersonate the Responder of the exchange and
send a forged Commit payload after receiving the Initiator's Commit.
The attacker then waits until it receives the authentication payload
from the Responder. Now the attacker can attempt to run through all
possible values of the pre-shared key, computing SKE (see
Section 8.2), computing "ss" (see Section 8.4.3), and attempting to
recreate the Confirm payload from the Responder.
But the attacker committed to a single guess of the pre-shared key
with her forged Commit. That value was used by the Responder in his
computation of "ss" which was used in the authentication payload.
Any guess of the pre-shared key which differs from the one used in
the forged Commit would result in each side using a different secret
element in the computation of "ss" and therefore the authentication
payload could not be verified as correct, even if a subsequent guess,
while running through all possible values, was correct. The attacker
gets one guess, and one guess only, per active attack.
An attacker, acting as either the Initiator or Responder, can take
the Element from the Commit message received from the other party,
reconstruct the random "mask" value used in its construction and then
recover the other party's "private" value from the Scalar in the
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Commit message. But this requires the attacker to solve the discrete
logarithm problem which we assumed was intractable above (Section 7).
Instead of attempting to guess at pre-shared keys an attacker can
attempt to determine SKE and then launch an attack. But SKE is
determined by the output of the pseudo-random function, prf, which is
assumed to be indistinguishable from a random source (Section 7).
Therefore, each element of the finite cyclic group will have an equal
probability of being the SKE. The probability of guessing SKE will
be 1/r, where r is the order of the group. This is the same
probability of guessing the solution to the discrete logarithm which
is assumed to be intractable (Section 7). The attacker would have a
better chance of success at guessing the input to prf, i.e. the pre-
shared key, since the order of the group will be many orders of
magnitude greater than the size of the pool of pre-shared keys.
The implications of resistance to dictionary attack are significant.
An implementation can provision a pre-shared key in a practical and
realistic manner-- i.e. it MAY be a character string and it MAY be
relatively short-- and still maintain security. The nature of the
pre-shared key determines the size of the pool, D, and
countermeasures can prevent an adversary from determining the secret
in the only possible way: repeated, active, guessing attacks. For
example, a simple four character string using lower-case English
characters, and assuming random selection of those characters, will
result in D of over four hundred thousand. An adversary would need
to mount over one hundred thousand active, guessing attacks (which
will easily be detected) before gaining any significant advantage in
determining the pre-shared key.
If an attacker knows the number of hunting-and-pecking loops that
were required to determine SKE, it is possible to eliminate passwords
from the pool of potential passwords and increase the probability of
successfully guessing the real password. MODP groups will require
more than "n" loops with a probability based on the value of the
prime-- if m is the largest unsigned number that can be expressed in
len(p) bits then the probability is ((m-p)/p)^n-- which will
typically be very small for the groups defined in [IKEV2-IANA]. ECP
groups will require more than one "n" loops with a probability of
roughly (1-(r/2p))^n. Therefore, a security parameter, k, is defined
that will ensure that at least k loops will always be executed
regardless of whether SKE is found in less than k loops. There is
still a probability that a password would require more than k loops,
and a side-channel attacker could use that information to his
advantage, so selection of the value of k should be based on a trade-
off between the additional work load to always perform k iterations
and the potential of providing information to a side-channel
attacker. It is important to note that the possibility of a
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successful side channel attack is greater against ECP groups than
MODP groups and it might be appropriate to have separate values of k
for the two.
For a more detailed discussion of the security of the key exchange
underlying this authentication method see [SAE] and [RFC5931].
11. Acknowledgements
The author would like to thank Scott Fluhrer and Hideyuki Suzuki for
their insight in discovering flaws in earlier versions of the key
exchange that underlies this authentication method and for their
helpful suggestions in improving it. Thanks to Lily Chen for useful
advice on the hunting-and-pecking technique to "hash into" an element
in a group and to Jin-Meng Ho for a discussion on countering a small
sub-group attack. Rich Davis suggested several checks on received
messages that greatly increase the security of the underlying key
exchange. Hugo Krawczyk suggested using the prf as an extractor.
12. References
12.1. Normative References
[IKEV2-IANA]
"Internet Assigned Numbers Authority, IKEv2 Parameters",
.
[RFC2104] Krawczyk, H., Bellare, M., and R. Canetti, "HMAC: Keyed-
Hashing for Message Authentication", RFC 2104,
February 1997.
[RFC2119] Bradner, S., "Key words for use in RFCs to Indicate
Requirement Levels", BCP 14, RFC 2119, March 1997.
[RFC3454] Hoffman, P. and M. Blanchet, "Preparation of
Internationalized Strings ("stringprep")", RFC 3454,
December 2002.
[RFC4013] Zeilenga, K., "SASLprep: Stringprep Profile for User Names
and Passwords", RFC 4013, February 2005.
[RFC5996] Kaufman, C., Hoffman, P., Nir, Y., and P. Eronen,
"Internet Key Exchange Protocol Version 2 (IKEv2)",
RFC 5996, September 2010.
[RFC6090] McGrew, D., Igoe, K., and M. Salter, "Fundamental Elliptic
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Curve Cryptography Algorithms", RFC 6090, February 2011.
[RFC6467] Kivinen, T., "Secure Password Framework for Internet Key
Exchange Version 2 (IKEv2)", RFC 6467, December 2011.
12.2. Informative References
[BM92] Bellovin, S. and M. Merritt, "Encrypted Key Exchange:
Password-Based Protocols Secure Against Dictionary
Attack", Proceedings of the IEEE Symposium on Security and
Privacy, Oakland, 1992.
[BMP00] Boyko, V., MacKenzie, P., and S. Patel, "Provably Secure
Password Authenticated Key Exchange Using Diffie-Hellman",
Proceedings of Eurocrypt 2000, LNCS 1807 Springer-Verlag,
2000.
[BPR00] Bellare, M., Pointcheval, D., and P. Rogaway,
"Authenticated Key Exchange Secure Against Dictionary
Attacks", Advances in Cryptology -- Eurocrypt '00, Lecture
Notes in Computer Science Springer-Verlag, 2000.
[RFC4086] Eastlake, D., Schiller, J., and S. Crocker, "Randomness
Requirements for Security", BCP 106, RFC 4086, June 2005.
[RFC4301] Kent, S. and K. Seo, "Security Architecture for the
Internet Protocol", RFC 4301, December 2005.
[RFC5869] Krawczyk, H. and P. Eronen, "HMAC-based Extract-and-Expand
Key Derivation Function (HKDF)", RFC 5869, May 2010.
[RFC5931] Harkins, D. and G. Zorn, "Extensible Authentication
Protocol (EAP) Authentication Using Only a Password",
RFC 5931, August 2010.
[SAE] Harkins, D., "Simultaneous Authentication of Equals: A
Secure, Password-Based Key Exchange for Mesh Networks",
Proceedings of the 2008 Second International Conference on
Sensor Technologies and Applications Volume 00, 2008.
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Author's Address
Dan Harkins
Aruba Networks
1322 Crossman Avenue
Sunnyvale, CA 94089-1113
United States of America
Email: dharkins@arubanetworks.com
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