# Explicit Exclusive Set Systems with Applications David P. Woodruff Joint work with Craig Gentry and Zulfikar Ramzan.

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Explicit Exclusive Set Systems with Applications David P. Woodruff Joint work with Craig Gentry and Zulfikar Ramzan

Outline 1. The Combinatorics Problem 2. Our Techniques 3. Applications 1. Broadcast encryption 2. Certificate revocation 3. Group testing

The Combinatorics Problem Find a family C of subsets of {1, 2, …., n} such that any large set S µ {1, 2, …, n} is the union of a small number of sets in C S = S 1 [ S 2 [ [ S t Parameters: Universe is [n] = {1, …, n} |S| >= n-r Write S as a union of · t sets in C Goal: Minimize |C|

The Combinatorics Problem Find a family C of subsets of [n] such that any set S µ [n] with |S| ¸ n-r is union of t sets in C: S = S 1 [ S 2 [ [ S t Example: t = 1 C = all sets of size ¸ n-r |C| = Example: t = n C = all sets of size 1 |C| = n C excludes sets of size · r C is an exclusive set system

Another Example Example: r = 1, t = 2 Write each i 2 [n] as (i 1, i 2 ) 2 [n 1/2 ] 2 x S: 1 i n … excludes 1st coordinate i 1 = excludes 2nd coordinate i 2 |C| = 2n 1/2

Another Example (Generalized) r = 1, t · log n Write each i 2 [n] as (i 1, i 2, …, i t ) 2 [n 1/t ] t Sets in C are named (x, y) 2 [t] x [n 1/t ] i 2 (x,y) iff i x y |C| = tn 1/t If S = [n] n i, S = (1, i 1 ) [ (2, i 2 ) [ … [ (t, i t )

Example Summary r arbitrary t = 1: |C| = t = n: |C| = n t · log n r = 1: |C| = tn 1/t How does |C| grow given n, r, and t?

A Lower Bound Claim: 1. At least sets of size ¸ n-r 2. Only different unions 3. Thus, 4. Solve for |C| Proof:

Example Summary r arbitrary t = 1: |C| = t = n: |C| = n t · log n r = 1: |C| = tn 1/t tight What happens for arbitrary n, r, and t?

Known Results Bad: once n and r are chosen, t and |C| are fixed t|C|authors (r log n / log r) 2 GSY r log n/r2nLNN, ALO 2rn log nLNN r 3 log n / log r KRS

Known Results Only known general result: If r · t, then |C| = O(t 3 (nt) r/t log n) [KR] Drawbacks: Probabilistic method Set-Cover To write S = S 1 [ S 2 [ … [ S t, solve Set-Cover C has large description Bad for applications Suboptimal size:

Our Results Main result: |C| = poly(r,t) n, r, t all arbitrary Match lower bound up to poly(r,t) In applications r, t << n When r,t << n, get |C| = O(rt ) Our construction is explicit Find sets S = S 1 [ … [ S t in poly(r, t, log n) time Improved cryptographic applications

Outline 1. The Combinatorics Problem 2. Our Techniques 3. Applications 1. Broadcast encryption 2. Certificate revocation 3. Group testing

Techniques Case analysis: r, t << n: algebraic solution general r, t: use divide-and-conquer approach to reduce to previous case

Case: r,t << n Find a prime p = n 1/t + Integers [n] are points in (F p ) t Consider the ring F p [X 1, …, X t ] Goal: find set of polynomials C such that for any R ½ [n] with |R| · r, there exist p 1, …, p t 2 C such that R = Variety(p 1, …, p t )

The Polynomial Collection Consider the following collection: and

The Polynomial Collection (Cond) and Claim: If no two points in R have the same ith coordinate for any i, then we can find p 1, …, p t with Variety(p 1, …, p t ) = R Proof: choose j=1 |R| (X 1 – u j 1 ) let u i 1, u i 2, …, u i |R| be the ith coordinates and u i+1 1, u i+1 2, …, u i+1 |R| be the (i+1)st coordinates choose p i+1 = f(X i ) – X i+1 by interpolating from f(u i j ) = u i+1 j for all j

The Polynomial Collection (Cond) Proof: choose j=1 |R| (X 1 – u j 1 ) let u i 1, u i 2, …, u i |R| be the ith coordinates and u i+1 1, u i+1 2, …, u i+1 |R| be the (i+1)st coordinates choose p i+1 = f(X i ) – X i+1 by interpolating from f(u i j ) = u i j+1 for all j Claim 1: Every point in R is in Variety(p 1, …, p t ) Proof: Induction. If x in variety, x 1 = u 1 j for some j p i+1 (x) = f(x i ) – x i+1 = 0 so: f(x i ) = f(u i j ) = u i+1 j = x i+1 Claim 2: If x 2 [n] n R, then x not in Variety(p 1, …, p t ) Proof: Immediate

The Polynomial Collection (Cond) |C| = O(tp r ), where p = n 1/t + Density theorems ! |C| = O(tn r/t ) Only works if R has distinct coordinates… and

Handling Non-distinct Coordinates Perform coordinate tranformations Each u 2 [n] is a degree-(t-1) polynomial p u in F p [x] Translate polynomial representation to point representation by evaluation: p u -> (p u (1), p u (2), …, p u (t)) p u p u implies translations are distinct Idea: choose many transformations (sets of t points in F p ), so every R has a transformation with distinct coordinates Apply previous construction

Handling Non-distinct Coordinates 1 2 3 … t (t+1) (t+2) … 2t (2t+1) … … Suppose R = {1, …, r} p1p2p3…prp1p2p3…pr 1 2 3 … t 2 2 3 … t 3 2 3 … t r 2 3 … t (t+1) (t+2) … 2t(2t+1) … … …

Handling Non-Distinct Coordinates How many blocks of t points do we need to consider? Two distinct degree-(t-1) polynomials can agree on at most t-1 points. Thus, at most can have non-distinct coordinates So choose blocks, apply distinct coordinate construction for each block Take union of constructions for all blocks

Summary and Improvements O(r 2 t) blocks, each O(t n r/t ) sets O(r 2 t 2 n r/t ) sets in total! Can improve to O(rt )

Improvements Choose special points in F p for blocks Mix the blocks with an expander Balance complexity of two types of sets

General n, r, t 1n Let m be such that r/m, t/m << n For every interval [i, j], form an exclusive set system with n = j-i+1, r = r/m, t = t/m Given a set R, find intervals which evenly partition R. ij x x x Problem! n 2 term ?!? Fix:- hash [n] to [r 2 ] first - do enough hashes so there is an injective hash for every R - apply construction above on [r 2 ]

Outline 1. The Combinatorics Problem 2. Our Techniques 3. Applications 1. Broadcast encryption 2. Certificate revocation 3. Group testing

Broadcast Encryption Server Clients 1 server, n clients Server broadcasts to all clients at once E.g., payperview TV, music, videos Only privileged users can understand broadcasts E.g., those who pay their monthly bills Need to encrypt broadcasts Offline phase - Server distributes keys Online phase - Server encrypts a session key so only privileged users can decrypt

Subset Cover Framework [NNL] Offline stage: For some S ½ [n], server creates a key K(S) and distributes it to all users in S Idea: choose sets S from an exclusive set system C Server space complexity ~ |C| ith user space complexity ~ # S containing i

Subset Cover Framework [NNL] Online stage: Given a set R ½ [n] of at most r revoked users Server establishes a session key M that only users in the set [n] n R know Finds S 1, …, S t with [n] n R = S 1 [ … [ S t Encrypt M under each of K(S 1 ), …, K(S t ) For u 2 [n] n R, there is S i with u 2 S i For u 2 R, no S i with u 2 S i Content encrypted using session key M

Subset Cover Framework [NNL] Online stage: Communication complexity ~ t Tolerate up to r revoked users Tolerate any number of colluders Information-theoretic security

Our Results Use our explicit exclusive set system General n,r,t Contrasts with previous explicit systems Poly(r,t, log n) time to find keys for broadcast Contrasts with probabilistic constructions Parameters For poly(r, log n) server storage complexity, we can set t = r log (n/r), but previously t = (r 2 log n)

More Reasons to Study Exclusive Sets Other applications Certificate revocation Group testing Fun mathematical problem

Open problems O(rt ) versus (t ) Our O(rt ) bound needs t = o(log n) Bound for general r,t is poly(r,t) Improve the poly(r,t) factor Find more applications

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