From this paper - "It has been proved that approximate SVP within a quasipolynomial factor is NP-hard under the randomized reduction." So is that, approximating the approximate SVP?
When will we find out if approximating the approximation of approximate SVP is NP-hard (under the randomized reduction, of course)?
One one hand, it's not really a crypto question -- it could equally well be about any C API that deals with dynamic memory allocation. On the other hand, the API is from a crypto standard.
I'm kind of thinking no... let's see how others feel.
@user474632 There seem to be a few quantifiers missing from the introduction there. I'd phrase it something like: A family of distributions $D_n$ is pseudorandom if, for any non-zero polynomial function $p$, there exists an $n_0$ such that $n \ge n_0 \implies | Pr[C(x)=1 | x∈U] − Pr[C(x)=1 | x∈D_n] | ≤ |1/p(n)|$.
...where $x∈D_n$ denotes that $x$ is a random variable (or maybe a sequence of variables?) sampled from the distribution $D_n$ (and should probably be written $x \sim D_n$, to be correct), and $U$ is the uniform distribution.
Sorry, I kind of used $D_n$ for two things there. What I meant is that $D_n$ is, for each $n$, a probability distribution -- and the collection $D = \langle D_n \rangle_n$ of these distributions is pseudorandom if it satisfies this property.
Basically, you can think of $n$ as something like the length of the possible keys used to generate the pseudorandom values; the larger the keyspace, the harder it is (or should be) to distinguish the distribution from random.
I'm not sure I follow... $C(x)$ is, by definition, 0 or 1, and $Pr[C(x)=1]$ could be anything between 0 and 1. The hard part is designing a circuit $C$ such that $C(x)=1$ significantly more often when $x$ is sampled from $D_n$ and not from $U$.
(That is, that's the hard part if you're trying to show that $D$ is not pseudorandom; if you're trying to show that it is, then the hard part is showing that there cannot be such a circuit $C$.)
Well, that's (somewhat) explained in the next section. Basically, the generator takes in a seed of $n$ bits (for some reason, the article switches the index from $n$ to $l$ there) and spits out an output stream of $m > n$ bits.
For which the generator has to scramble the bits from the uniform distribution such that the attacker can't identify the information from the pseudorandom bit..
Simple rearrangements of bit position aren't going to work, so I'm more interested in how that one pseudorandom bit gets scattered across the distribution