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Zero Knowledge and Circuit Minimization. Joint work with Bireswar Das (IIT Gandinagar, DIMACS). MFCS, Budapest, August 26, 2014. The Cook-Levin Theorem. SAT is NP-Complete. Arguably the most important theorem in theoretical computer science. …but what were they thinking?. - PowerPoint PPT Presentation
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Eric AllenderRutgers University
Zero Knowledge and Circuit Minimization
Zero Knowledge and Circuit Minimization
Joint work with Bireswar Das
(IIT Gandinagar, DIMACS)
MFCS, Budapest, August 26, 2014
Eric Allender: Zero Knowledge and Circuit Minimization < 2 >
The Cook-Levin TheoremThe Cook-Levin Theorem
Arguably the most important theorem
in theoretical computer science.
…but what were they thinking?
SAT is NP-Complete
Eric Allender: Zero Knowledge and Circuit Minimization < 3 >
What they were thinking:What they were thinking:
The STOC deadline
is nearly here…
Eric Allender: Zero Knowledge and Circuit Minimization < 4 >
What they were thinking:What they were thinking:
Looks like I wont be
able to prove a Graph
Isomorphism result in time…
So I’ll just submit this.
Eric Allender: Zero Knowledge and Circuit Minimization < 5 >
What they were thinking:What they were thinking:
I refuse to publish a partial
result! I need to be
able to say something about
the Minimum Circuit Size
Problem…
Eric Allender: Zero Knowledge and Circuit Minimization < 6 >
What they were thinking:What they were thinking:
…and Graph Isomorphism
too!
[Pemmaraju, Skiena]
Eric Allender: Zero Knowledge and Circuit Minimization < 7 >
What they were thinking:What they were thinking:
…and Graph Isomorphism
too!Leonid,
Publish it!
Eric Allender: Zero Knowledge and Circuit Minimization < 8 >
What they were thinking:What they were thinking:
OK…But only the 2-page version!
Eric Allender: Zero Knowledge and Circuit Minimization < 9 >
NP-Intermediate ProblemsNP-Intermediate Problems
Thus, as long as there has been a theory of NP-completeness, there have been two prominent candidates for “NP-Intermediate” status: in NP, but neither complete nor in P:
– Graph Isomorphism (GI)
– The Minimum Circuit Size Problem (MCSP) After 4 decades, they still cling to this status. …but is there any relationship between these
problems?
Eric Allender: Zero Knowledge and Circuit Minimization < 10 >
Graph IsomorphismGraph Isomorphism
GI = {(G,H) : the vertices of G can be permuted, to yield H}
Eric Allender: Zero Knowledge and Circuit Minimization < 11 >
MCSPMCSP
MCSP = {(x,i) : x is the truth table of a function with a circuit of size at most i}.
Why was Levin so interested in MCSP? In the USSR in the 70’s (and before) there
was great interest in problems requiring “perebor”, or “brute-force search”. For various reasons, MCSP was a focal point of this interest.
Eric Allender: Zero Knowledge and Circuit Minimization < 12 >
MCSPMCSP
MCSP = {(x,i) : x is the truth table of a function with a circuit of size at most i}.
Why was Levin so interested in MCSP? Yablonski [1959] proved a result that – to him
and his students – meant “MCSP requires perebor”. (This would imply P < NP.) By the late 1960’s Yablonski “attained influential positions [dealing with] coordination and control of math…a time of rapid degradation of the moral climate within the Soviet math community” [Trakhtenbrot].
Eric Allender: Zero Knowledge and Circuit Minimization < 13 >
GI and MCSPGI and MCSP
This historical digression has established: The questions of the complexity of GI and
MCSP are as old as the theory of computational complexity (or perhaps even older).
No relationship between the complexity of these problems had been established.
Let’s take care of that right now.
Eric Allender: Zero Knowledge and Circuit Minimization < 14 >
Today’s GoalToday’s Goal
Theorem 1: GI reduces to MCSP. More precisely: GI є RPMCSP.
Theorem 2: More generally: Every problem with a Statistical Zero Knowledge Proof reduces to MCSP. That is: SZK is contained in BPPMCSP.
We’ll follow a well-established path: All reductions to MCSP seem to make use of pseudorandom generators. [Kabanets, Cai] [A,Buhrman,Koucky,van Melkebeek, Ronneburger]
Eric Allender: Zero Knowledge and Circuit Minimization < 15 >
Pseudorandom GeneratorsPseudorandom Generators
For any efficient “test” T,
Prob[T accepts a random string of length n]
≈
Prob[T accepts a pseudorandom string of length n]
PseudoRandom bits b1,b2,…seed
G
Eric Allender: Zero Knowledge and Circuit Minimization < 16 >
Pseudorandom GeneratorsPseudorandom Generators
[HILL]: Given a cryptographically-
secure one-way function f,
we can build a secure
pseudorandom generator Gf.
PseudoRandom bits b1,b2,…seedGf
Eric Allender: Zero Knowledge and Circuit Minimization < 17 >
Pseudorandom GeneratorsPseudorandom Generators
[HILL]: If Gf is not secure,
then f is easy to invert.
PseudoRandom bits b1,b2,…seedGf
Eric Allender: Zero Knowledge and Circuit Minimization < 18 >
Pseudorandom GeneratorsPseudorandom Generators
[HILL]: If T is a test that accepts half of the
strings of length n, but accepts none of the
strings output by Gf,
then there is a probabilistic poly-time N such
that Probx[f(NT(f(x))) = f(x)] > 1/poly.
PseudoRandom bits b1,b2,…seedGf
Eric Allender: Zero Knowledge and Circuit Minimization < 19 >
Pseudorandom GeneratorsPseudorandom Generators
[HILL]: If T is a test that accepts half of the
strings of length n, but accepts none of the
strings output by Gfi,
then there is a probabilistic poly-time N such
that Probx[fi(NT(i,fi(x))) = x] > 1/poly.
PseudoRandom bits b1,b2,…seedGfi
Eric Allender: Zero Knowledge and Circuit Minimization < 20 >
Pseudorandom GeneratorsPseudorandom Generators
The output of Gfi has small time-bounded K-complexity.
PseudoRandom bits b1,b2,…seedGfi
Eric Allender: Zero Knowledge and Circuit Minimization < 21 >
Pseudorandom GeneratorsPseudorandom Generators
The output of Gfi has small time-bounded K-complexity.
KT(x) ≈ Circuit.size(x).
PseudoRandom bits b1,b2,…seedGfi
Eric Allender: Zero Knowledge and Circuit Minimization < 22 >
Pseudorandom GeneratorsPseudorandom Generators
The output of Gfi has small time-bounded K-complexity.
KT(x) ≈ Circuit.size(x).
Most x require very large circuits.
PseudoRandom bits b1,b2,…seedGfi
Eric Allender: Zero Knowledge and Circuit Minimization < 23 >
Pseudorandom GeneratorsPseudorandom Generators
The output of Gfi has small time-bounded K-complexity.
KT(x) ≈ Circuit.size(x).
Most x require very large circuits.
MCSP gives us a great test T to distinguish random
and pseudorandom strings.
PseudoRandom bits b1,b2,…seedGfi
Eric Allender: Zero Knowledge and Circuit Minimization < 24 >
Pseudorandom GeneratorsPseudorandom Generators
Specifically, the set
T = {x | Circuit.Size(x) >√|x|}
is computable relative to MCSP
and breaks all pseudorandom generators.
PseudoRandom bits b1,b2,…seedGfi
Eric Allender: Zero Knowledge and Circuit Minimization < 25 >
Pseudorandom GeneratorsPseudorandom Generators
Specifically, the set
T = {x | Circuit.Size(x) >√|x|}
is computable relative to MCSP
and breaks all pseudorandom generators.
Thus Probx[fi(NMCSP(i,fi(x))) = f(x)] > 1/poly.
PseudoRandom bits b1,b2,…seedGfi
Eric Allender: Zero Knowledge and Circuit Minimization < 26 >
Pseudorandom GeneratorsPseudorandom Generators
This idea was used before, to show:
Factoring is in ZPPMCSP
Discrete Log is in BPPMCSP
Closest Vector Problem is in BPPMCSP
PseudoRandom bits b1,b2,…seedGfi
We suspect that these are crypto-secure.
Eric Allender: Zero Knowledge and Circuit Minimization < 27 >
Reducing GI to MCSPReducing GI to MCSP
The main idea of the reduction is to follow this same approach, using a function that has never seemed like a good candidate for a one-way function.
Eric Allender: Zero Knowledge and Circuit Minimization < 28 >
Our Indexed Family of FunctionsOur Indexed Family of Functions
Given graph H and permutation π, let fH(π) = π(H).
To find out if G and H are isomorphic:
– Pick a random permutation π.
– Run NMCSP(H, π(G)) and obtain output β.
– Accept if π(G) = β(H). If G and H are isomorphic, this accepts with
probability 1/poly(n). QED!
Eric Allender: Zero Knowledge and Circuit Minimization < 29 >
Zero KnowledgeZero Knowledge
The Graph Isomorphism problem was one of the first few problems known to have a Zero Knowledge Interactive Proof.
Eric Allender: Zero Knowledge and Circuit Minimization < 30 >
Zero KnowledgeZero Knowledge
The Graph Isomorphism problem was one of the first few problems known to have a Zero Knowledge Interactive Proof.
NPcoNP
SZKGI
MCSP
Eric Allender: Zero Knowledge and Circuit Minimization < 31 >
Some facts about SZKSome facts about SZK
SZK is contained in NP/poly ∩ coNP/poly. There are complete problems for SZK. …but in order to introduce these complete
problems, we need to talk about “promise problems”.
Eric Allender: Zero Knowledge and Circuit Minimization < 32 >
Promise ProblemsPromise Problems
Ordinary decision problems.
Yes No
Eric Allender: Zero Knowledge and Circuit Minimization < 33 >
Promise ProblemsPromise Problems
Ordinary decision problems.
Yes No
Promise Problems.
Yes Don’t Care No
Eric Allender: Zero Knowledge and Circuit Minimization < 34 >
Statistical DifferenceStatistical Difference
The “standard” complete promise problem for SZK is Statistical Difference (SD).
The inputs to SD are pairs of circuits (C,D); we view the circuits as representing probability distributions, where ProbC(y) is the probability, over x chosen uniformly at random, that C(x)=y.
The Yes Instances of SD are (C,D) such that these probability distributions are quite close.
The No Instances of SD are (C,D) where the distributions are far apart.
Eric Allender: Zero Knowledge and Circuit Minimization < 35 >
Image Intersection DensityImage Intersection Density
We will actually use a restricted version of SD, called Image Intersection Density (IID). The Yes instances look the same as in SD.
The No instances are pairs (C,D) such that, with probability exponentially close to 1 (over randomly chosen x) C(x) is not in the image of D.
IID was shown by [Ben-Or, Gutfreund] to be complete for a subclass of SZK, which was subsequently shown to coincide with SZK [Chailloux, Ciodan, Kerenidis, Vadhan].
Eric Allender: Zero Knowledge and Circuit Minimization < 36 >
Reducing SZK to MCSPReducing SZK to MCSP
For any circuit C, let FC(x) = C(x). These are the “one-way functions” that we’ll try to invert, with MCSP as an oracle.
Given a pair (C,D), repeat the following K times:
– Pick x at random, and compute y=C(x).
– Run NMCSP(D, y) and obtain output z.
– Accept if D(z) = y. On Yes instances, we expect K/poly
acceptances,
Eric Allender: Zero Knowledge and Circuit Minimization < 37 >
Reducing SZK to MCSPReducing SZK to MCSP
For any circuit C, let FC(x) = C(x). These are the “one-way functions” that we’ll try to invert, with MCSP as an oracle.
Given a pair (C,D), repeat the following K times:
– Pick x at random, and compute y=C(x).
– Run NMCSP(D, y) and obtain output z.
– Accept if D(z) = y. On Yes instances, we expect K/poly
acceptances, on No instances we expect K/2n.
Eric Allender: Zero Knowledge and Circuit Minimization < 38 >
Reducing SZK to MCSPReducing SZK to MCSP
For any circuit C, let FC(x) = C(x). These are the “one-way functions” that we’ll try to invert, with MCSP as an oracle.
Given a pair (C,D), repeat the following K times:
– Pick x at random, and compute y=C(x).
– Run NMCSP(D, y) and obtain output z.
– Accept if D(z) = y. On Yes instances, we expect K/poly
acceptances, on No instances we expect K/2n.
QED
Eric Allender: Zero Knowledge and Circuit Minimization < 39 >
How hard is MCSP?How hard is MCSP?
Eric Allender: Zero Knowledge and Circuit Minimization < 40 >
How hard is MCSP?How hard is MCSP?
[Kabanets, Cai] showed that if MCSP were NP-complete under “natural” ≤m reductions, then BPP=P.
This is not evidence against being NP-complete, but it is evidence that it might be hard to prove.
Vinodchandran considered SNCMP (like MCSP but for “strong nondeterministic circuits”); it will be a breakthrough if GI reduces to SNCMP under “natural” reductions.
…but our argument provides an RP-reduction!
Eric Allender: Zero Knowledge and Circuit Minimization < 41 >
Open QuestionsOpen Questions
Is GI in ZPPMCSP? …or in PMCSP? …or is MCSP NP-hard, perhaps under P/poly
reductions?
– Note in this regard, that the “Minimum QBF Circuit Size Problem” is complete for PSPACE under P/poly reductions, and analogous results hold for other classes.
Eric Allender: Zero Knowledge and Circuit Minimization < 42 >
Open QuestionsOpen Questions
Or is there a promise problem related to MCSP that is complete for SZK?
Consider the promise problem that has:
– Yes instances: {x | Circuit.Size(x) >√|x|}
– No instances: {x | Circuit.Size(x) <|x|1/4} Can this problem be in SZK? Or in some
other “nearby” class?
Eric Allender: Zero Knowledge and Circuit Minimization < 43 >
Thank you!Thank you!