CertSGN

We will briefly describe here the contributions of the article, in which members of the certSign research group introduced a new method for producing the following:

• Starting with an encryption scheme which is homomorphic with respect to one operation (such as multiplication), the recipe of the authors produces another encryption scheme which is now homomorphic with respect to two operations (for example, addition and multiplication).

The authors use this technique to construct examples of encryption schemes that, theoretically can handle any algebraic function on encrypted data.

The homomorphic encryption scheme CSGN, a symmetric homomorphic encryption scheme with plaintext $\mathbb {F} _{2}$ (the field with two elements) was introduced in the same article. The latter plays an essential role the architecture of a privacy-preserving contact tracing application, developed by certSign as part of the TAMEC project.

The content of the article is protected under the law by two patents.

Ring homomorphic encryption schemes from monoidal ones. The blueprint

Given a monoid $M$ and any commutative ring $R$ with unity, one can associate to these an algebra $R[M]$. As an $R$-module, the monoid algebra $R[M]$ is free with a basis consisting of the symbols $[x]$, where $x\in M$.

The multiplication in this algebra is defined by extending $[x]\cdot [y]=[xy]$ in an $R$-bilinear manner. Any element $a\in R[M]$ has a unique representation

$a=\sum _{x\in M}a_{x}[x],$

where $a_{x}=0$ for all but finitely many $x\in M$. The product of two elements $a,b\in R[M]$ is given by

$ab=\sum _{x\in M}\left(\sum _{yz=x}a_{y}b_{z}\right)[x].$

We note that the identity element with respect to multiplication is $1[e]$, where $e$ is the identity element of $M$. If $M$ is a group then the monoid algebra described above is called a group algebra.

If $M,N$ are two monoids, a monoid homomorphism $\phi :M\to N$ induces a natural $R$-algebra homomorphism $\phi _{R}:R[M]\to R[N]$.

We also remark that for any $R$-algebra $A$, there is a natural $R$-algebra homomorphism $\epsilon :R[A]\to A$ given by

$\epsilon \left(\sum _{x\in R}r_{x}[x]\right)=\sum _{x\in R}r_{x}x$.

The patented blueprint

Let $R$ be a finite ring and let $(G,H,E,D)$ be a monoid homomorphic encryption scheme. This implies that the ciphertext $G$ and the plaintext $H$ are monoids and the decryption algorithm $D:G\to H$ is a monoid homomorphism.

Consider an efficiently computable $R$-character $\chi :H\to A$, where $A$ is a finite $R$-algebra.

As explained above, the monoid homomorphism $D:G\to H$ induces the $R$-algebra homomorphism $D_{R}:R[G]\to R[H]$. At the same time, $\chi$ induces an $R$-algebra homomorphism $\chi _{R}:R[H]\to R[A]$. The $R$-algebra homomorphism $\mathrm {Dec}$ is defined as

$\mathrm {Dec} =\epsilon \circ \chi _{R}\circ D_{R}:R[G]\to R[H]\to R[A]\to A$,

defined by the formula

$\mathrm {Dec} \left(\sum _{g\in G}a_{g}[g]\right)=\sum _{g\in G}a_{g}\chi (D(g))$.

Let us denote by $S$ the image of $\chi$ in $A$. For the decryption algorithm to remain secure, one needs the assumption that $\chi$ is not the trivial character, a condition that is always assumed in the blueprint.

We now describe a ring homomorphic encryption scheme with plaintext $A$ and ciphertext $R[G]$. Let $S$ be the image of $\chi$ in $A$ and fix some integer $k\geq 1$ such that the elements of the form $\sum _{i=1}^{k}r_{i}s_{i}$, with $s_{i}\in S$ is the whole $R$-algebra $A$.

• $\mathrm {Enc} :$ Consider a fixed tuple $(r_{1},\dots ,r_{k})\in R^{k}$. For a plaintext $m\in A$ consider $(h_{1},\dots ,h_{k})\in H^{k}$ such that $m=\sum _{i=1}^{k}r_{i}\chi (h_{i})$. Then

$\mathrm {Enc} (m)=\sum _{i=1}^{k}r_{i}[E(h_{i})]$ .

• $\mathrm {Dec} :$ The decryption algorithm is given by

$\mathrm {Dec} \left(\sum _{g\in G}a_{g}[g]\right)=\sum _{g\in G}a_{g}\chi (D(g)).$

The authors of the article prove that $(R[G],R,\mathrm {Enc} ,\mathrm {Dec} )$ is a ring homomorphic encryption scheme and the security of this scheme is the same as the security of the monoid encryption scheme $(G,H,E,D)$ that one starts with.

A symmetric ring homomorphic encryption scheme

In this section we describe the CertSGN scheme. As ciphertext space we take $G=\mathbb {F} _{2}^{n}$, where we consider the monoid structure defined by component-wise multiplication. Basically, $G$ is the commutative monoid generated by $n$ idempotents with no other relations between these. As plaintext, we consider the monoid $\mathbb {F} _{2}$. The CertSGN scheme is defined as follows:

• Setup($1^{\lambda }$): Choose the dimension parameter $n=n(\lambda )$ and the integers $d=d(\lambda )$, $s=s(\lambda )$ such that $n=2sd$.

• SecretKeygen: Choose a subset $S$ of $\{1,2,\dots ,n\}$ of size $s$. Set the secret key to be $S$.

• $E:$ To encrypt a bit $m\in \mathbb {F} _{2}$, choose $d$ random numbers $i_{1},i_{2},\dots ,i_{d}$ from the set $\{1,2,\dots ,n\}$ such that there are exactly $m$ of them in the secret key $S$. Set $E(m)$ to be the vector in $G$, whose components corresponding to the indices $i_{1},i_{2},\dots ,i_{d}$ are equal to $0$ and the others are equal to $1$.

• $D$: To decrypt a ciphertext $c\in \mathbb {F} _{2}^{n}$, set $D(c)=0$ if $c$ has at least one component equal to $0$ corresponding to an index from $S$ and $D(c)=1$ otherwise.

Remark that if one represents the secret key as the indicator vector of $S$, namely ${\overline {s}}\in \mathbb {F} _{2}^{n}$ then the decryption algorithm $D$ can be expressed as an inner product over $\mathbb {F} _{2}$ between $c$ and ${\overline {s}}$.

We refer to the paper [1] for a proof of the correction of this scheme and for security and efficiency analyses.