Blom's scheme

Blom's scheme is a symmetric threshold key exchange protocol in cryptography. The scheme was proposed by the Swedish cryptographer Rolf Blom in a series of articles in the early 1980s.^[1]^[2]

A trusted party gives each participant a secret key and a public identifier, which enables any two participants to independently create a shared key for communicating. However, if an attacker can compromise the keys of at least k users, he can break the scheme and reconstruct every shared key. Blom's scheme is a form of threshold secret sharing.

Blom's scheme is currently used by the HDCP (Version 1.x only) copy protection scheme to generate shared keys for high-definition content sources and receivers, such as HD DVD players and high-definition televisions. A generalized multicast version of the scheme, and a lower bound for such schemes (including Blom's) was given in ^[3]

The protocol

The key exchange protocol involves a trusted party (Trent) and a group of $\scriptstyle n$ users. Let Alice and Bob be two users of the group.

Protocol setup

Trent chooses a random and secret symmetric matrix $\scriptstyle D_{k,k}$ over the finite field $\scriptstyle GF(p)$ , where p is a prime number. $\scriptstyle D$ is required when a new user is to be added to the key sharing group.

For example:

${\begin{aligned}k&=3\\p&=17\\D&={\begin{pmatrix}1&6&2\\6&3&8\\2&8&2\end{pmatrix}}\ \mathrm {mod} \ 17\end{aligned}}$

Inserting a new participant

New users Alice and Bob want to join the key exchanging group. Trent chooses public identifiers for each of them; i.e., k-element vectors:

$I_{\mathrm {Alice} },I_{\mathrm {Bob} }\in GF^{k}(p)$ .

For example:

$I_{\mathrm {Alice} }={\begin{pmatrix}1\\2\\3\end{pmatrix}},I_{\mathrm {Bob} }={\begin{pmatrix}5\\3\\1\end{pmatrix}}$

Trent then computes their private keys:

${\begin{aligned}g_{\mathrm {Alice} }&=DI_{\mathrm {Alice} }\\g_{\mathrm {Bob} }&=DI_{\mathrm {Bob} }\end{aligned}}$

Using $D$ as described above:

${\begin{aligned}g_{\mathrm {Alice} }&={\begin{pmatrix}1&6&2\\6&3&8\\2&8&2\end{pmatrix}}{\begin{pmatrix}1\\2\\3\end{pmatrix}}={\begin{pmatrix}19\\36\\24\end{pmatrix}}\ \mathrm {mod} \ 17={\begin{pmatrix}2\\2\\7\end{pmatrix}}\ \\g_{\mathrm {Bob} }&={\begin{pmatrix}1&6&2\\6&3&8\\2&8&2\end{pmatrix}}{\begin{pmatrix}5\\3\\1\end{pmatrix}}={\begin{pmatrix}25\\47\\36\end{pmatrix}}\ \mathrm {mod} \ 17={\begin{pmatrix}8\\13\\2\end{pmatrix}}\ \end{aligned}}$

Each will use their private key to compute shared keys with other participants of the group.

Computing a shared key between Alice and Bob

Now Alice and Bob wish to communicate with one another. Alice has Bob's identifier $\scriptstyle I_{\mathrm {Bob} }$ and her private key $\scriptstyle g_{\mathrm {Alice} }$ .

She computes the shared key $\scriptstyle k_{\mathrm {Alice/Bob} }=g_{\mathrm {Alice} }^{T}I_{\mathrm {Bob} }$ , where $\scriptstyle T$ denotes matrix transpose. Bob does the same, using his private key and her identifier, giving the same result:

$k_{\mathrm {Alice/Bob} }=k_{\mathrm {Alice/Bob} }^{T}=(g_{\mathrm {Alice} }^{T}I_{\mathrm {Bob} })^{T}=(I_{\mathrm {Alice} }^{T}D^{T}I_{\mathrm {Bob} })^{T}=I_{\mathrm {Bob} }^{T}DI_{\mathrm {Alice} }=k_{\mathrm {Bob/Alice} }$

They will each generate their shared key as follows:

${\begin{aligned}k_{\mathrm {Alice/Bob} }&={\begin{pmatrix}2\\2\\7\end{pmatrix}}^{T}{\begin{pmatrix}5\\3\\1\end{pmatrix}}=2\times 5+2\times 3+7\times 1=23\ \mathrm {mod} \ 17=6\\k_{\mathrm {Bob/Alice} }&={\begin{pmatrix}8\\13\\2\end{pmatrix}}^{T}{\begin{pmatrix}1\\2\\3\end{pmatrix}}=8\times 1+13\times 2+2\times 3=40\ \mathrm {mod} \ 17=6\end{aligned}}$

Attack resistance

In order to ensure at least k keys must be compromised before every shared key can be computed by an attacker, identifiers must be k-linearly independent: all sets of k randomly selected user identifiers must be linearly independent. Otherwise, a group of malicious users can compute the key of any other member whose identifier is linearly dependent to theirs. To ensure this property, the identifiers shall be preferably chosen from a MDS-Code matrix (maximum distance separable error correction code matrix). The rows of the MDS-Matrix would be the identifiers of the users. A MDS-Code matrix can be chosen in practice using the code-matrix of the Reed–Solomon error correction code (this error correction code requires only easily understandable mathematics and can be computed extremely quickly).^[4]

References

↑ Blom, Rolf. Non-public key distribution. In Proc. CRYPTO 82, pages 231–236, New York, 1983. Plenum Press
↑ Blom, Rolf. "An optimal class of symmetric key generation systems", Report LiTH-ISY-I-0641, Linköping University, 1984
↑ Carlo Blundo, Alfredo De Santis, Amir Herzberg, Shay Kutten, Ugo Vaccaro, Moti Yung: Perfectly-Secure Key Distribution for Dynamic Conferences. CRYPTO 1992: 471-486
↑ Menezes, A; Paul C. van Oorschot & Scott A. Vanstone (1996). Handbook of Applied Cryptography. CRC Press. ISBN 0-8493-8523-7.

This article is issued from Wikipedia. The text is licensed under Creative Commons - Attribution - Sharealike. Additional terms may apply for the media files.