using nondeterminism to amplify hardness emanuele viola joint work with: alex healy and salil vadhan...
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Using Nondeterminism to Amplify Hardness
Emanuele Viola
Joint work with: Alex Healy and Salil Vadhan
Harvard University
Average-Case Hardness of NP
• Study hardness of NP on random instances– Natural question, essential for cryptography
• One Goal: relate worst-case & avg-case hardness– Done for #P, PSPACE, EXP... [L89, BF90, BFL91, ...]– New techniques needed for NP [FF91, BT03, V03, V04]
• This Talk: hardness amplification– Relate mild avg-case & strong avg-case hardness
Hardness Amplification
• Def: f : {0,1}n ! {0,1} is -hard for size s if
8 circuit C of size s Prx[C(x) f(x)] ¸
HardnessAmplification
e.g., -hardfor size s
e.g., -hard
for size ¼ s
where = (n´)
f f 0
Standard Hardness Amplification
• Yao’s XOR Lemma:
f : {0,1}n ! {0,1} -hard for size s = s(n)
) f 0(x1, . . ., xk) = f(x1) © . . . © f(xk)
• k = n ) n´ = n2 and f 0 : {0,1}n' ! {0,1}
• ¼ Optimal, but cannot use in NP:
f 2 NP ; f 0 2 NP
O’Donnell’s Amplification in NP
• Idea: f´(x1, . . ., xk) = C(f(x1), . . ., f(xk)), C monotone
• e.g. f(x1) Æ ( f(x2) Ç f(x3) ). Then f´ 2 NP if f 2 NP
• Theorem [O’Donnell `02]: 9 balanced f 2 NP (1/poly(n))-hard for size n(1)
) 9 f´ 2 NP -hard for size (n´)(1)
• Barrier: No such construction can amplify above
Thm: 9 balanced f 2 NP (1/poly(n))-hard for size s(n)
) 9 f´ 2 NP ¼ -hard for size ¼
Examples:
– s(n) = n(1) ) hardness
– s(n) = 2n(1) ) hardness
– s(n) = 2(n) ) hardness
Our Main Result
Approach• Obs: Hardness of f´(x1, . . ., xk) = C(f(x1), . . ., f(xk))
limited by
• Idea 1: Derandomization [I95, IW97]
for “pseudorandom” generator G, so
• E.g. if then hope f´ -hard
• Q: Why does this still amplify hardness? – We exhibit unconditional G s.t. this works
f´() = C(f(x1), . . ., f(xk)) , where (x1,...,xk) = G()
Approach (cont.)
• Q: How to compute f´2 NP when k = (n´)(1)?
• Idea 2: Nondeterminism
– Use C s.t. C(f(x1), . . ., f(xk)) can be computed
nondeterministically looking at only log(k) f(xi )’s.
– So f´2 NP even when k = 2n’
f´() = C(f(x1), . . ., f(xk)) , where (x1,...,xk) = G()
Outline
• Trevisan’s (2003) proof of O’Donnell’s theorem
• Identify properties of G that suffice & find such G
• Describe C ensuring f´ 2 NP
• Negative results:
balanced f and nondeterminism necessary
f´()=C(f(x1), . . ., f(xk)) , where (x1,...,xk)=G()
Notation
• f : {0,1}n ! {0,1} -hard for size s (e.g. =.01, s = 2(n))
• f´(x1, . . ., xk) := C(f(x1), . . ., f(xk)) for appropriate monotone C
• Aim: Show f´ has hardness ¼ 1/2 - 1/k for size s´ = k = s(1)
Step 1: Hardcore Lemma [Imp95]
• f -hard ) indistinguishable from F w/ coin-flip on 2 frac. of inputs
0 1coin-flip
2 frac.
0 1 ¼f F
• Formally: no circuit of size s´ can distinguish (x,f(x)) from (x,F(x)) for random x w/ advantage > 1/s´
Step 2: Info-theoretic hardness
0 1coin-flip
2 frac.
0 1 ¼f F
(x,f(x)) ´ (x,F(x))
) (x1,....,xk,f(x1),...,f(xk)) ´ (x1,...,xk,F(x1),...,F(xk))
) Hardness of C(f(x1),...,f(xk)) for size s´ ¼ hardness of C(F(x1),...,F(xk)) for size s´ ¸ hardness of C(F(x1),...,F(xk)) for size 1
uses independence
Step 3: Noise Sensitivity
0 1coin-flip
2 frac.
0 1 ¼f F
• Info-theoretic hardness of C(F(x1),...,F(xk)) depends only on C and !
• Hardness ¼ NoiseSens[C]
where i = 1 independently with probability
uses independence
Step 4: Choosing C
• There is monotone C : {0,1}k ! {0,1}
) C(f(x1), . . ., f(xk)) has hardness ¼ 1/2 - 1/k
• The barrier [KKL88]: 8 monotone C : {0, 1}k ! {0, 1},
Outline
• Trevisan’s (2003) proof of O’Donnell’s theorem
• Identify properties of G that suffice & find such G
• Describe C ensuring f´ 2 NP
• Negative results:
balanced f and nondeterminism necessary
f´()=C(f(x1), . . ., f(xk)) , where (x1,...,xk)=G()
Step 2: Info-theoretic hardness
0 1coin-flip
2 frac.
0 1 ¼f F
(x,f(x)) ´ (x,F(x))
) (x1,....,xk,f(x1),...,f(xk)) ´ (x1,...,xk,F(x1),...,F(xk))
) Hardness of C(f(x1),...,f(xk)) for size s´ ¼ hardness of C(F(x1),...,F(xk)) for size s´ ¸ hardness of C(F(x1),...,F(xk)) for size 1
uses independence
Preserving Indistinguishability
(x,f(x)) ´ (x,F(x)) ) (x1,....,xk,f(x1),...,f(xk)) ´ (x1,...,xk,F(x1),...,F(xk))
• Want: G to be indistinguishability-preserving:
(x,f(x)) ´ (x,F(x)) ) (,f(x1),...,f(xk)) ´ (,F(x1),...,F(xk)) where (x1,...,xk)=G()
• Achieved via combinatorial designs [Nis91,NW94].
Step 3: Noise Sensitivity
0 1coin-flip
2 frac.
0 1 ¼f F
• Info-theoretic hardness of C(F(x1),...,F(xk)) depends only on C and !
• Hardness ¼ NoiseSens[C]
where i = 1 independently with probability
uses independence
• Want:
• Show 9 randomized constant-depth circuit s.t. 8 x1,...,xk
• Use existence of unconditional G against constant-depth circuits [Nis90]
Fooling Noise Sensitivity
¼
C
x1 x2 . . . . xk
F ...
C
F F F ...F F
A has constant depth and size(A) = poly(2n,k) (using C constant depth and size(C) = poly(k))
A
Want:
Nisan’s Pseudorandom Generator
• Want Pr[A(x1, . . ., xk) = 1] ¼ Pr[A(G()) = 1]
• Theorem [Nis91]: There is G : {0,1}logO(1) N ! {0,1}N such that above holds for every A of size N and constant depth
• Recall size(A) = poly(2n,k) ) Input length of Nisan’s generator is poly(n), even for k = 2n
Completing Derandomization• Let G(1,2) = Gind-pres(1) © Gconst-depth(2)
• f´()=C(f(x1), . . ., f(xk)) , where (x1,...,xk)=G()
• Thm: f´ has hardness ¼ 1/2 - 1/k for size s´ = k = s(1)
• n´ = O(n2) (w/PRG vs space [Nis91]) ) hardness
Outline
• Trevisan’s (2003) proof of O’Donnell’s theorem
• Identify properties of G that suffice & find such G
• Describe C ensuring f´ 2 NP
• Negative results:
balanced f and nondeterminism necessary
f´()=C(f(x1), . . ., f(xk)) , where (x1,...,xk)=G()
The Structure of C
C = TRIBES MONOTONE DNF [BL90]
Claim: If f 2 NP then f´ 2 NP even for k = 2n´
Proof: To compute f´():– Guess a clause, say (f(xi+1) Æ . . . Æ f(xi+b))
– Check if clause is true
Thm: 9 balanced f 2 NP (1/poly(n))-hard for size s(n)
) 9 f´ 2 NP ¼ -hard for size ¼
Examples:
– s(n) = n(1) ) hardness
– s(n) = 2n(1) ) hardness
– s(n) = 2(n) ) hardness
Our Main Result
Balanced Functions• Both our results and O’Donnell’s
need balanced f 2 NP. That is:
• Theorem: Any monotone “black-box” hardness amplification cannot amplify beyond
• Proof Idea:– “Black-box” hardness amplification ) error correcting code
[I02,TV02,V03,T03]
– Good monotone codes only exist for balanced messages[Kruskal-Katona]
Nondeterminism is Necessary
• Use of nondeterminism is likely to be necessary
• Theorem: There is no deterministic, monotone “black-box” hardness amplification that amplifies beyond
• Our amplification is nondeterministic, monotone, black-box, and amplifies up to
Conclusion• O’Donnell’s hardness amplification in NP:
– Amplifies up to– No construction of same form does better
• Our result: amplify up to
• Two new techniques:1. Derandomization G fools noise sensitivity
2. Nondeterminism k = n(1)
• Only obstacle to hardness is PRG with
logarithmic seed length for space or const-depth