By Sanjay Burman (auth.), Marc Joye, Debdeep Mukhopadhyay, Michael Tunstall (eds.)

ISBN-10: 3642245862

ISBN-13: 9783642245862

This e-book constitutes the refereed lawsuits of the 1st foreign convention on defense facets in details know-how, High-Performance Computing and Networking held in Haldia, India, in October 2011. The 14 complete papers provided including the abstracts of two invited lectures have been conscientiously reviewed and chosen from 112 sumbissions. The papers tackle all present elements in cryptography, safeguard points in excessive functionality computing and in networks to boot. The papers are divided in topical sections on embedded protection; electronic rights administration; cryptographic protocols; cryptanalysis/side channel assaults; and cipher primitives.

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Additional info for Security Aspects in Information Technology: First International Conference, InfoSecHiComNet 2011, Haldia, India, October 19-22, 2011. Proceedings

Example text

The computation of lT,U (x, y) is the main weakness of pairing computation over Fp against side-channel attacks. The DPA attack described above can easily find out the x and y-coordinates of private point SID by exploiting the above formula. The main drawback of the above formula is that the public and private parameters are directly involved to perform an Fp operation. The side-channel attack thus exploit the respective Fp operation for finding out the secret bits by manipulating public parameter U .

If we assume that Fp squaring (s) ≈ Fp multiplication (m) then the cost of above operations is 6m on a programmable core in our dual-core PCP. At the same time other core starts the computation of f 2 . We represent the Miller function f ∈ F((p2 )3 )2 as : (f0,0 +f0,1 V +f0,2 V 2 )+(f0,0 +f0,1 V +f0,2 V 2 )W, where fi,j ∈ Fp2 . The equivalent representations of f are : f = f0 + f1 W, wheref0 , f1 ∈ Fp6 ; f ∈ F(p6 )2 . = (f0,0 + f0,1 V + f0,2 V 2 ) + (f1,0 + f1,1 V + f1,2 V 2 )W, wherefi,j ∈ Fp2 ; f ∈ F((p2 )3 )2 .

Let us assume that all operations are performed on 2’s complement numbers. Therefore, the subtraction k k−1 k−1 ¯ 2i +1, S = x−X2 could be performed as: S = i=0 2i si = i=0 2i xi + i=0 2i X ¯ 2i corresponds to where k represents the bit length of operands (x, X2 ) and X the 1’s complement of X2i . The subtraction is started from the least significant bit (or LSB) by computing sum and carry bits iteratively. The formula for i-th ¯ 2i ⊕ xi ci−1 ⊕ X ¯ 2i ci−1 . Similarly, the i-th sum bit is carry bit is: ci = xi X ¯ computed as: si = xi ⊕ X2i ⊕ ci−1 for k − 1 ≤ i ≤ 0 with c−1 = 1.

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Security Aspects in Information Technology: First International Conference, InfoSecHiComNet 2011, Haldia, India, October 19-22, 2011. Proceedings by Sanjay Burman (auth.), Marc Joye, Debdeep Mukhopadhyay, Michael Tunstall (eds.)

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