Abstract
There are natural cryptographic applications where an adversary only gets to tamper a high-speed data stream on the fly based on her view so far, namely, the lookahead tampering model. Since the adversary can easily substitute transmitted messages with her messages, it is farfetched to insist on strong guarantees like error-correction or, even, manipulation detection. Dziembowski, Pietrzak, and Wichs (ICS–2010) introduced the notion of non-malleable codes that provide a useful message integrity for such scenarios. Intuitively, a non-malleable code ensures that the tampered codeword encodes the original message or a message that is entirely independent of the original message.
Our work studies the following tampering model. We encode a message into \(k\geqslant 1\) secret shares, and we transmit each share as a separate stream of data. Adversaries can perform lookahead tampering on each share, albeit, independently. We call this k-lookahead model.
First, we show a hardness result for the k-lookahead model. To transmit an \(\ell \)-bit message, the cumulative length of the secret shares must be at least \(\frac{k}{k-1}\ell \). This result immediately rules out the possibility of a solution with \(k=1\). Next, we construct a solution for 2-lookahead model such that the total length of the shares is \(3\ell \), which is only 1.5x of the optimal encoding as indicated by our hardness result.
Prior work considers stronger model of split-state encoding that creates \(k\geqslant 2\) secret shares, but protects against adversaries who perform arbitrary (but independent) tampering on each secret share. The size of the secret shares of the most efficient 2-split-state encoding is \(\ell \log \ell /\log \log \ell \) (Li, ECCC–2018). Even though k-lookahead is a weaker tampering class, our hardness result matches that of k-split-state tampering by Cheraghchi and Guruswami (TCC–2014). However, our explicit constructions above achieve much higher efficiency in encoding.
H. K. Maji—The research effort is supported in part by an NSF CRII Award CNS–1566499, an NSF SMALL Award CNS–1618822, and an REU CNS–1724673.
H. K. Maji and M. Wang—The research effort is supported in part by a Purdue Research Foundation grant.
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Notes
- 1.
Concurrent and independent work of [21] obtained similar result.
- 2.
- 3.
Specifically, in their proof of Theorem 5.3, they picked two messages \(s_0\), \(s_1\) along with \(X_\eta \) that satisfy the property we require for \(m_0\), \(m_1\) in the imported lemma. Also, we stress that their proof not only showed \(s_0\) and \(s_1\) exist, but there are multiple choices for the pair. This gives us the freedom when we pick our \(m_0\) and \(m_1\). We make use of this in our proof.
- 4.
We note that such codewords would exist otherwise we can show that the last bit of the first state is redundant for decoding. This way we can obtain a smaller encoding. Then, w.l.o.g., we can apply our argument on this new encoding.
- 5.
Specifically, Theorem 30 in [2] states that there exists a constant-rate non-malleable reduction from 2-split-state tampering family to the following tampering function family consisting of union of split-state lookahead and forgetful tampering functions.
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Gupta, D., Maji, H.K., Wang, M. (2018). Non-malleable Codes Against Lookahead Tampering. In: Chakraborty, D., Iwata, T. (eds) Progress in Cryptology – INDOCRYPT 2018. INDOCRYPT 2018. Lecture Notes in Computer Science(), vol 11356. Springer, Cham. https://doi.org/10.1007/978-3-030-05378-9_17
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