Patent Application: US-201214377499-A

Abstract:
in the present disclosure , implementations of diffie - hellman key agreement are provided that , when embodied in software , resist extraction of cryptographically sensitive parameters during software execution by white - box attackers . four embodiments are taught that make extraction of sensitive parameters difficult during the generation of the public key and the computation of the shared secret . the embodiments utilize transformed random numbers in the derivation of the public key and shared secret . the traditional attack model for diffie - hellman implementations considers only black - box attacks , where attackers analyze only the inputs and outputs of the implementation . in contrast , white - box attacks describe a much more powerful type of attacker who has total visibility into the software implementation as it is being executed .

Description:
fig1 illustrates the process of key pair generation for our proposed white - box elliptic curve diffie - hellman ( wb - ecdh ) implementation , in accordance with a first embodiment of the present disclosure . fig2 illustrates the process of shared secret computation . each static and ephemeral private key d and public key q shall be generated using the appropriate domain parameters , d , which must be selected from one of the two sets of domain parameters specified in the list of suite b elliptic curves and domain parameters ( see appendix a of [ 7 ]). henceforth , we assume that domain parameters have been appropriately selected . compute q = dg without disclosing d inside the memory of one party &# 39 ; s machine , where q = dg =( r + 1 ) g , r is the random number . q is the public key , and may represent any one of q e , a , q e , b or q s , b depending on the particular ecdh scheme ( eu - ecdh or op - ecdh ). d is the private key , and , similarly , it may represent any one of d e , a , d e , b or d s , b . in this embodiment , the transformation t of a random number r is denoted as { circumflex over ( r )} and defined as { circumflex over ( r )}= t ( r )= k 1 r + k 2 mod n , where k 1 and k 2 are two instance - specific , compile time , random numbers and k 1 , k 2 εz n * ( note that z n * denotes the set of integers in the range 1 to n − 1 that are relatively prime to the domain parameter n ). thus , { circumflex over ( r )}= k 1 r + k 2 mod n and r = k 1 − 1 { circumflex over ( r )}− k 2 k 1 − 1 mod n . it is important to note that the output of the random bit generator ( rbg ) used in key pair generation is interpreted as producing transformed random numbers . this means that the transformation t ( r ) does not have to be explicitly applied by the implementation — the transformation is implicit in the way in which the output of the rbg is interpreted . once the instance - specific , compile time , random numbers k 1 and k 2 are selected , two auxiliary elliptic curve points are pre - computed : ĝ = k 1 − 1 g and u 2 =( k 1 − k 2 ) ĝ . these two points are computed during an off - line set - up phase where the implementation is not subject to white - box attacks ( e . g . at compilation time ). 1 . status : the status returned from the key pair generation procedure . the status will indicate success or an error . 2 . { circumflex over ( r )} a transformed random number . 3 . q : the generated public key . 1 . set n = len ( n ) ( i . e . set n equal to the bit length of the domain parameter n ). check that n is valid , that is , n = 256 or n = 384 ( the only valid lengths for suite b ). 2 . if n is invalid , then return an error indication . 3 . set requested_security_strength = the security strength associated with n ( either 128 when using p - 256 or 192 when using p - 384 ). 4 . obtain a string of n bits ( b ′ 1 , b ′ 2 , . . . , b ′ n ) from a random bit generator ( rbg ) with a security strength of requested_security_strength or more , which generates the transformed random number { circumflex over ( r )}= k 1 r + k 2 mod n . if an error indication is returned , then return the error indication . 5 . compute u 1 ={ circumflex over ( r )} ĝ ( recall that ĝ = k 1 − 1 g was precomputed ). 6 . compute q = u 1 + u 2 ( recall that u 2 =( k 1 − k 2 ) ĝ was precomputed ). it can be shown that the previous procedure produces a public key that is compatible with the original procedure given in [ 7 ]. the original procedure produces a public key q =( r + 1 ) g ; for the new procedure , we have in our proposed key pair generation procedure , the cost of elliptic curve computations is as follows . three elliptic curve point multiplications are required , two of which are offline and one is online . one elliptic curve point addition is required . party a computes the shared secret z , which is the x - coordinate of an elliptic curve point , using the appropriate domain parameters d , party b &# 39 ; s public key ( q b ), and their transformed random number { circumflex over ( r )} a . party b computes the shared secret in an analogously , using party a &# 39 ; s public key and their own transformed random number . we continue compute p =( r a + 1 ) q b without disclosing r a ( party a &# 39 ; s random number ) inside the memory of party a &# 39 ; s machine . let k 1 ( a ) and k 2 ( a ) denote party a &# 39 ; s instance - specific , compile time , random numbers . party a should pre - compute the integer values s = k 1 ( a ) − 1 mod n and t = k 1 ( a ) − k 2 ( a ) mod n . these two values are computed during an off - line set - up phase where the implementation is not subject to white - box attacks ( e . g . at compilation time ). if party b &# 39 ; s public key is known in advance , as is the case in op - ecdh , then further pre - computation can be done . when doing op - ecdh , the elliptic curve points { circumflex over ( q )} b 1 = sq b = k 1 ( a ) − 1 q b and { circumflex over ( q )} b 3 = t { circumflex over ( q )} b 1 =( k 1 ( a ) − k 2 ( a ) ){ circumflex over ( q )} b 1 should be computed off - line . 1 . { circumflex over ( r )} a : party a &# 39 ; s transformed random number ( recall that r a = k 1 ( a ) − 1 { circumflex over ( r )} a − k 2 ( a ) k 1 ( a ) − 1 mod n ). 2 . q b : the other party &# 39 ; s ( party b ) public key . 1 . compute points { circumflex over ( q )} b 1 = sq b = k 1 ( a ) − 1 q b ; { circumflex over ( q )} b 2 ={ circumflex over ( r )} a { circumflex over ( q )} b 1 ; and { circumflex over ( q )} b 3 = t { circumflex over ( q )} b 1 =( k 1 ( a ) − k 2 ( a ) ){ circumflex over ( q )} b 1 2 . compute p ={ circumflex over ( q )} b 2 +{ circumflex over ( q )} b 3 3 . if p = o , the point at infinity , output an error indicator . 4 . z = x p where x p is the x - coordinate of p . it can be shown that the previous procedure , which is summarized in fig2 , produces a shared secret that is compatible with the original procedure given in [ 7 ]. the original procedure produces a shared secret equal to ( r a + 1 ) q b ; for the new procedure , we have in our proposed shared secret computation procedure , the cost of elliptic curve computations is as follows . three elliptic curve point multiplications required . for op - ecdh , two of the point multiplications are off - line and one is online ; for eu - ecdh , all three point multiplications are online . one elliptic curve point addition is required . the second embodiment of the disclosure is a reduced version of the first embodiment . the second embodiment is described with reference to fig3 and 4 . the main concern in this design is computational efficiency . compute q = dg without disclosing d inside the memory of one party &# 39 ; s machine . in this embodiment , the transformation of the random number r is defined as { circumflex over ( r )}= t ( r )= k 1 r mod n , where k 1 is an instance specific , compile time random number selected from the set z n *. thus , { circumflex over ( r )}= k 1 r mode and r = k 1 − 1 { circumflex over ( r )} mod n . once the instance - specific , compile time , random number k 1 is selected , an auxiliary elliptic curve point is pre - computed : ĝ = k 1 − 1 g . as in the first embodiment , this point should be computed during an off - line set - up phase where the implementation is not subject to white - box attacks ( e . g . at compilation time ). input and output are the same as that of the first embodiment . 1 . steps 1 , 2 and 3 are the same as of the first embodiment . 4 . obtain a string of n bits ( b ′ 1 , b ′ 2 , . . . , b ′ n ) from a random bit generator ( rbg ) with a security strength of requested_security_strength or more , which generates the transformed random number { circumflex over ( r )}= k 1 r mod n . if an error indication is returned , then return the error indication . 5 . compute u 1 ={ circumflex over ( r )} ĝ ( recall that ĝ = k 1 − 1 g was pre - computed ). 6 . compute q = u 1 + g 7 . return success , { circumflex over ( r )} and q . the following sequence of identities show that the previous procedure produces a public key that is compatible with the original procedure given in [ 7 ]: the costs of elliptic curve computations for key pair generation are now as follows . two elliptic curve point multiplications are required ( one online and one offline ). one elliptic curve point addition is required . we explain shared secret computation from the perspective of party a . party a will use the appropriate domain parameters d , the other party &# 39 ; s public key ( q b ), and their transformed random number { circumflex over ( r )} a to compute z , which is the x - coordinate of an elliptic curve point p . compute p =( r a + 1 ) q b without disclosing r a inside the memory of party a &# 39 ; s machine . let k 1 ( a ) denote party a &# 39 ; s instance - specific , compile time , random number . party a should pre - compute the integer values s = k 1 ( a ) − 1 mod n . this value should be computed during an off - line set - up phase where the implementation is not subject to white - box attacks ( e . g . at compilation time ). if party b &# 39 ; s public key is known in advance , as is the case in op - ecdh , then further pre - computation can be done . when doing op - ecdh , the elliptic curve point { circumflex over ( q )} b = sq b = k 1 ( a ) − 1 q b should be computed off - line . 1 . { circumflex over ( r )} a : party a &# 39 ; s transformed random number ( recall that r a = k 1 ( a ) − 1 { circumflex over ( r )} a mod n ). 2 . q b : the other party &# 39 ; s ( party b ) public key . 1 . compute points { circumflex over ( q )} b 1 = sq b = k 1 ( a ) − 1 q b ; and { circumflex over ( q )} b 2 ={ circumflex over ( r )} a { circumflex over ( q )} b 1 2 . p ={ circumflex over ( q )} b 2 + q b 3 . if p = o , the point at infinity , output an error indicator . 4 . z = x p where x p is the x - coordinate of p . it can be shown that the previous procedure , which is summarized in fig4 , produces a shared secret that is compatible with the original procedure given in [ 7 ]. consider the following sequence of identities : the costs of elliptic curve computations for shared secret computation are now as follows . two elliptic curve point multiplications are required . for op - ecdh , one point multiplication is off - line and one is online . for eu - ecdh , both point multiplications are online . one elliptic curve point addition is required ( for both op - ecdh and eu - ecdh ). the second embodiment is a reduced version of the first embodiment . one instance specific random number is removed from the first embodiment , which reduces the number of elliptic curve computations , but possibly sacrifices security strength . this methodology is suitable for those applications where computational efficiency is a prime concern . the third embodiment is described with reference to fig5 and 6 . the third embodiment is an enhanced version of the first embodiment where security strength is a prime concern . the computational cost of this embodiment is higher . compute q = dg without disclosing d inside the memory of one party &# 39 ; s machine . in this methodology , the random bit generator generates two transformed random numbers { circumflex over ({ circumflex over ( r )} 11 and { circumflex over ({ circumflex over ( r )} 22 that , in combination , encode two random numbers r i and r 2 . the resultant public key , q , may be generated using either r 1 or r 2 , and this choice may be made at runtime within the key pair generation procedure . thus , our proposed procedure can compute q = dg =( r 1 + 1 ) g or q = dg =( r 2 + 1 ) g . the values { circumflex over ({ circumflex over ( r )} 11 and { circumflex over ({ circumflex over ( r )} 22 output by the rbg are interpreted as being produced by two layers of transformations . one layer corresponds to the same transformation technique of the first embodiment ; namely , a linear transform using instance specific , compile time random numbers drawn from the set z n *. the second layer is a pseudo - hadamard transformation [ 11 ], which ensures that r 1 and r 2 can only be recovered from the combination of both { circumflex over ({ circumflex over ( r )} 11 and { circumflex over ({ circumflex over ( r )} 22 . more precisely , { circumflex over ({ circumflex over ( r )} 11 and { circumflex over ({ circumflex over ( r )} 22 are interpreted as follows : { circumflex over ({ circumflex over ( r )} 11 ={ circumflex over ( r )} 1 +{ circumflex over ( r )} 2 mod 2 n { circumflex over ({ circumflex over ( r )} 22 ={ circumflex over ( r )} 1 + 2 { circumflex over ( r )} 2 mod 2 n we interpret { circumflex over ({ circumflex over ( r )} 11 and { circumflex over ({ circumflex over ( r )} 22 as being the result of a pseudo - hadamard transform applied to the values { circumflex over ( r )} 1 and { circumflex over ( r )} 2 . note that n is equal to the bit length of the domain parameter n , and { circumflex over ( r )} 1 and { circumflex over ( r )} 2 are transformed values that encode r 1 and r 2 respectively . to recover { circumflex over ( r )} 2 from { circumflex over ({ circumflex over ( r )} 11 and { circumflex over ({ circumflex over ( r )} 22 , we compute { circumflex over ({ circumflex over ( r )} 22 −{ circumflex over ({ circumflex over ( r )} 11 mod 2 n ; and to recover { circumflex over ( r )} 1 we compute 2 { circumflex over ({ circumflex over ( r )} 11 −{ circumflex over ({ circumflex over ( r )} 22 mod 2 n . the definition of { circumflex over ( r )} 1 and { circumflex over ( r )} 2 is { circumflex over ( r )} 1 = k 11 r 1 + k 12 mod n { circumflex over ( r )} 2 = k 21 r 2 + k 22 mod n here , k 11 , k 12 , k 21 , k 22 are instance specific , compile time random numbers drawn from the set z n *. as in the first embodiment , we have r 1 = k 11 − 1 { circumflex over ( r )} 1 − k 12 k 11 − 1 mod n and r 2 = k 21 − 1 { circumflex over ( r )} 2 − k 22 k 21 − 1 mod n . once the instance - specific , compile time , random numbers k 11 , k 12 , k 21 , k 22 are selected , two sets of auxiliary elliptic curve points are pre - computed : ĝ 11 = k 11 − 1 g , ĝ 12 = k 11 − 1 ĝ 11 , u 12 =( k 11 − k 12 ) ĝ 11 and ĝ 21 = k 21 − 1 g , ĝ 22 = k 21 − 1 ĝ 21 , u 22 =( k 21 − k 22 ) ĝ 21 . as in the first embodiment , these points should be computed during an off - line set - up phase where the implementation is not subject to white - box attacks ( e . g . at compilation time ). input and output are the same as that of the first embodiment . 1 . steps 1 , 2 and 3 are the same as that of the first embodiment . 4 . obtain strings of n bits ( b ′ 11 , b ′ 12 , . . . , b ′ in ) and ( b ′ 21 , b ′ 22 , . . . , b ′ 2n ) from a random bit generator ( rbg ) with a security strength of requested_security_strength or more , which generates the transformed random numbers { circumflex over ({ circumflex over ( r )} 11 =({ circumflex over ( r )} 1 +{ circumflex over ( r )} 2 ) mod 2 n and { circumflex over ({ circumflex over ( r )} 22 =({ circumflex over ( r )} 1 + 2 { circumflex over ( r )} 2 ) mod 2 n . if an error indication is returned , then return the error indication . 5 . if (“ r 1 ” is chosen ), then a . compute u 11 =( 2 { circumflex over ({ circumflex over ( r )} 11 −{ circumflex over ({ circumflex over ( r )} 22 mod 2 n ) k 11 mod n . b . compute q = u 11 ĝ 12 + u 12 ( recall that ĝ 12 and u 12 were pre - computed ) c . compute u 21 =({ circumflex over ({ circumflex over ( r )} 22 −{ circumflex over ({ circumflex over ( r )} 11 mod 2n ) k 21 . d . q = u 21 * ĝ 22 + u 22 ( recall that ĝ 22 and u 22 were pre - computed ) 7 . return success , { circumflex over ({ circumflex over ( r )} 11 , { circumflex over ({ circumflex over ( r )} 22 and q . the procedure is illustrated in fig5 and it can be verified that the resultant q is equal to either ( r 1 + 1 ) g or ( r 2 + 1 ) g as follows : we explain shared secret computation from the perspective of party a . party a will use the appropriate domain parameters d , the other party &# 39 ; s public key ( q b ), and their own transformed random numbers { circumflex over ({ circumflex over ( r )} 11 ( a ) ,{ circumflex over ({ circumflex over ( r )} 22 ( a ) to compute z . without disclosing r 1 ( a ) and r 2 ( a ) inside the memory of the party a &# 39 ; s machine , compute p =( r 1 ( a ) + 1 ) q b or p =( r 2 ( a ) + 1 ) q b depending on whether r 1 ( a ) + 1 or r 2 ( a ) + 1 was selected as party a &# 39 ; s private key . let k 11 ( a ) , k 12 ( a ) , k 21 ( a ) , k 22 ( a ) denote party a &# 39 ; s instance - specific , compile time , random numbers . party a should pre - compute the integer values s 1 = k 11 ( a ) − 1 mod n and s 2 = k 21 ( a ) − 1 mod n . these values should be computed during an off - line set - up phase where the implementation is not subject to white - box attacks ( e . g . at compilation time ). if party b &# 39 ; s public key is known in advance , as is the case in op - ecdh , then further pre - computation can be done . when doing op - ecdh , the elliptic curve points { circumflex over ( q )} b 11 = s 1 q b = k 11 ( a ) − 1 q b , { circumflex over ( q )} b 12 =( k 11 ( a ) − k 12 ( a ) ){ circumflex over ( q )} b 11 m { circumflex over ( q )} b 21 = s 2 q b = k 21 ( a ) − 1 q b , and { circumflex over ( q )} b 22 =( k 21 ( a ) − k 22 ( a ) ){ circumflex over ( q )} b 21 should be computed off - line . 1 . { circumflex over ({ circumflex over ( r )} 11 ( a ) ,{ circumflex over ({ circumflex over ( r )} 22 ( a ) : party a &# 39 ; s transformed random numbers . 2 . q b : the other party &# 39 ; s ( party b ) public key . a . compute { circumflex over ( q )} b 11 = s 1 q b , { circumflex over ( q )} b 12 =( k 11 ( a ) − k 12 ( a ) ){ circumflex over ( q )} b 11 and { circumflex over ( q )} b 13 =( 2 { circumflex over ({ circumflex over ( r )} 11 ( a ) −{ circumflex over ({ circumflex over ( r )} 22 ( a ) mod 2 n ){ circumflex over ( q )} b 11 ( recall that s 1 was pre - computed ). b . p ={ circumflex over ( q )} b 12 +{ circumflex over ( q )} b 13 c . if p = o , the point at infinity , output an error indicator . d . z = x p where x p is the x - coordinate of p . a . compute { circumflex over ( q )} b 21 = s 2 q b , { circumflex over ( q )} b 22 =( k 21 ( a ) − k 22 ( a ) ){ circumflex over ( q )} b 21 and { circumflex over ( q )} b 23 =({ circumflex over ({ circumflex over ( r )} 22 ( a ) −{ circumflex over ({ circumflex over ( r )} 11 ( a ) mod 2 n ){ circumflex over ( q )} b 21 ( recall that s 2 was pre - computed ). b . p ={ circumflex over ( q )} b 22 +{ circumflex over ( q )} b 23 c . if p = o , the point at infinity , output an error indicator . d . z = x p where x p is the x - coordinate of p . the procedure is illustrated in fig6 . the correctness of the procedure can be verified as follows : the third embodiment may be the most resistant to white - box attacker . in this embodiment , two random numbers use to make it more difficult for the attacker to follow the execution path of the program . furthermore , two transformations are used to mask the random numbers . as a result , computational efficiency is degraded . the third embodiment is suitable for those applications where security strength is the main concern . the fourth embodiment is described with reference to fig7 and 8 . the fourth embodiment is an enhanced version of the second embodiment . compute q = dg without disclosing d inside the memory of one party &# 39 ; s machine . as was done the in third embodiment , the fourth embodiment uses the random bit generator to generate two transformed random numbers { circumflex over ({ circumflex over ( r )} 11 and { circumflex over ({ circumflex over ( r )} 22 that , in combination , encode two random numbers r 1 and r 2 . the resultant public key , q , may be generated using either r 1 or r 2 , and this choice may be made at runtime within the key pair generation procedure . the values { circumflex over ({ circumflex over ( r )} 11 and { circumflex over ({ circumflex over ( r )} 22 output by the rbg are interpreted as being produced by two layers of transformations . one layer corresponds to the transformation technique of the second embodiment ; namely , a linear transform using instance specific , compile time random numbers drawn from the set z n *. the second layer is a pseudo - hadamard transformation , as in the third embodiment . more precisely , { circumflex over ({ circumflex over ( r )} 11 and { circumflex over ({ circumflex over ( r )} 22 are interpreted as follows : { circumflex over ({ circumflex over ( r )} 11 ={ circumflex over ( r )} 1 +{ circumflex over ( r )} 2 mod 2 n { circumflex over ({ circumflex over ( r )} 22 ={ circumflex over ( r )} 1 + 2 { circumflex over ( r )} 2 mod 2 n we interpret { circumflex over ({ circumflex over ( r )} 11 and { circumflex over ({ circumflex over ( r )} 22 as being the result of a pseudo - hadamard transform applied to the values { circumflex over ( r )} 1 and { circumflex over ( r )} 2 . note that n is equal to the bit length of the domain parameter n , and { circumflex over ( r )} 1 and { circumflex over ( r )} 2 are transformed values that encode r 1 and r 2 respectively . to recover { circumflex over ( r )} 2 from { circumflex over ( r )} 11 and { circumflex over ( r )} 22 , we compute { circumflex over ({ circumflex over ( r )} 22 −{ circumflex over ({ circumflex over ( r )} 11 mod 2 n ; and to recover { circumflex over ( r )} 1 we compute 2 { circumflex over ({ circumflex over ( r )} 11 −{ circumflex over ({ circumflex over ( r )} 22 mod 2 n . the definition of { circumflex over ( r )} 1 and { circumflex over ( r )} 2 is here , k 11 , k 21 are instance specific , compile time random numbers drawn from the set z n *. as in the second embodiment , we have r 1 = k 11 − 1 { circumflex over ( r )} 1 mod n and r 2 = k 21 − 1 { circumflex over ( r )} 2 mod n . once the instance - specific , compile time , random numbers k 11 , k 21 are selected , two sets of auxiliary elliptic curve points are pre - computed : ĝ 11 = k 11 − 1 g , ĝ 12 = k 11 − 1 ĝ 11 and ĝ 21 = k 21 − 1 g , ĝ 22 = k 21 − 1 ĝ 21 . as in the first embodiment , these points should be computed during an off - line set - up phase where the implementation is not subject to white - box attacks ( e . g . at compilation time ). input and output are the same as that of the third embodiment . 1 . steps 1 , 2 and 3 are the same as that of the first embodiment . 4 . obtain strings of n bits ( b ′ 11 , b ′ 12 , . . . , b ′ 1n ) and ( b ′ 21 , b ′ 22 , . . . , b ′ 2n ) from a random bit generator ( rbg ) with a security strength of requested_security_strength or more , which generates the transformed random numbers { circumflex over ({ circumflex over ( r )} 11 =({ circumflex over ( r )} 1 +{ circumflex over ( r )} 2 ) mod 2 n and { circumflex over ({ circumflex over ( r )} 22 =({ circumflex over ( r )} 1 + 2 { circumflex over ( r )} 2 ) mod 2 n . if an error indication is returned , then return the error indication , and invalid_q . 5 . if (“ r 1 ” is chosen ), then a . compute u 11 =( 2 { circumflex over ({ circumflex over ( r )} 11 −{ circumflex over ({ circumflex over ( r )} 22 mod 2 n ) k 11 b . compute q = u 11 ĝ 12 + g ( recall that ĝ 12 was pre - computed ). a . compute u 2i =({ circumflex over ({ circumflex over ( r )} 22 −{ circumflex over ({ circumflex over ( r )} 11 mod 2 n ) k 21 b . q = u 21 * ĝ 22 + g ( recall that ĝ 22 was pre - computed ). 7 . return success , { circumflex over ({ circumflex over ( r )} 11 , { circumflex over ({ circumflex over ( r )} 22 and q . the computational process is illustrated in fig7 . its correctness can be verified as follows : as before , we explain shared secret computation from the perspective of party a . party a will use the appropriate domain parameters d , the other party &# 39 ; s public key ( q b ), and their own transformed random numbers { circumflex over ({ circumflex over ( r )} 11 ( a ) ,{ circumflex over ({ circumflex over ( r )} 22 ( a ) to compute z . without disclosing r 1 ( a ) and r 2 ( a ) inside the memory of the party a &# 39 ; s machine , compute p =( r 1 ( a ) + 1 ) q b or p =( r 2 ( a ) + 1 ) q b depending on whether r 1 ( a ) + 1 or r 2 ( a ) + 1 was selected as party a &# 39 ; s private key . let k 11 ( a ) , k 21 ( a ) denote party a &# 39 ; s instance - specific , compile time , random numbers . party a should pre - compute the integer values s 1 = k 11 ( a ) − 1 mod n and s 2 = k 21 ( a ) − 1 mod n . these values should be computed during an off - line set - up phase where the implementation is not subject to white - box attacks ( e . g . at compilation time ). if party b &# 39 ; s public key is known in advance , as is the case in op - ecdh , then further pre - computation can be done . when doing op - ecdh , the elliptic curve points { circumflex over ( q )} b 11 = s 1 q b = k 11 ( a ) − 1 q b and { circumflex over ( q )} b 21 = s 2 q b = k 21 ( a ) − 1 q b should be computed off - line . 1 . { circumflex over ({ circumflex over ( r )} 11 ( a ) ,{ circumflex over ({ circumflex over ( r )} 22 ( a ) : party a &# 39 ; s transformed random numbers . 2 . q b : the other party &# 39 ; s ( party b ) public key . a . compute { circumflex over ( q )} b 11 = s 1 q b and { circumflex over ( q )} b 12 =( 2 { circumflex over ({ circumflex over ( r )} 11 ( a ) −{ circumflex over ({ circumflex over ( r )} 22 ( a ) mod 2 n ){ circumflex over ( q )} b 11 b . compute p ={ circumflex over ( q )} b 12 + q b c . if p = o , the point at infinity , output an error indicator . d . z = x p where x p is the x - coordinate of p . a . compute { circumflex over ( q )} b 21 = s 2 q b ; and { circumflex over ( q )} b 22 =({ circumflex over ({ circumflex over ( r )} 22 ( a ) −{ circumflex over ({ circumflex over ( r )} 11 ( a ) mod 2 n ){ circumflex over ( q )} b 21 b . compute p ={ circumflex over ( q )} b 2 + q b c . if p = o , the point at infinity , output an error indicator . d . z = x p where x p is the x - coordinate of p . the computational process is illustrated in fig8 . its correctness can be verified as follows : the fourth embodiment attempts to reach a compromise between security and computational efficiency . table a shows the computational comparison among the proposed white - box ecdh design embodiments . table a allows the four embodiments to be ranked in terms of their computational cost . the embodiments can also be approximately ranked in descending order of security strength as embodiment 3 , embodiment 1 , embodiment 4 , embodiment 2 . numerous modifications , variations and adaptations may be made to the particular embodiments described above without departing from the scope patent disclosure , which is defined in the claims . s . chow , p . eisen , h . johnson , p . c . van oorschot , “ white - box cryptography and an aes implementation ”, in nyberg , k ., heys , h . m ., eds . : selected areas in cryptography 2002 ( sac 2002 ), lecture notes in computer science ( lncs ), volume 2595 , springer verlag , pp . 250 - 270 , 2003 . s . chow , p . eisen , h . johnson , p . c . van oorschot , “ a white - box des implementation for drm applications ”, in proceedings of acm ccs - 9 workshop drm , springer , pp . 1 - 15 , 2002 . wb ecdsa , international patent application no . pct / ca2010 / 000486 filed mar . 31 , 2010 . wb sha , international patent application no . pct / ca2011 / 050172 filed mar . 31 , 2011 . w . diffie , m . hellman , “ new directions in cryptography ”, ieee transactions on information theory , vol . 22 , issue . 6 , pp . 644 - 654 , november 1976 . suite b implementer &# 39 ; 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( available at http :// www . nsa . gov / ia / _files / suiteb_implementer_g - 113808 . pdf ) standards for efficient cryptography ; “ sec 1 : elliptic curve cryptography , version 2 . 0 ”, contact : daniel r . l . brown , certicom research , © 2009 certicom corp , may 2009 . d . hankerson , a . menezes , s . vanstone , “ guide to elliptic curve cryptography ”, springer - verlag publication , isbn 0 - 387 - 95273 - x , 2004 . hitachi ltd ., intel corporation , panasonic corporation , sony corporation , toshiba corporation , “ digital transmission content protection specification volume 1 ( informational version )”, revision 1 . 7 , december , 2011 . james l . massey . “ safer k - 64 : a byte - oriented block - ciphering algorithm ”, in ross anderson , ed . : fast software encryption &# 39 ; 93 , lecture notes in computer science , volume 809 , springer verlag , pp . 1 - 17 , 1994 .