Given a finite set of points $P subseteq mathbb{R}^d$, we would like to find a small subset $S subseteq P$ such that the convex hull of $S$ approximately contains $P$. More formally, every point in $P$ is within distance $epsilon$ from the convex hull of $S$. Such a subset $S$ is called an $epsilon$-hull. Computing an $epsilon$-hull is an important problem in computational geometry, machine learning, and approximation algorithms. In many real world applications, the set $P$ is too large to fit in memory. We consider the streaming model where the algorithm receives the points of $P$ sequentially and strives to use a minimal amount of memory. Existing streaming algorithms for computing an $epsilon$-hull require $O(epsilon^{-(d-1)/2})$ space, which is optimal for a worst-case input. However, this ignores the structure of the data. The minimal size of an $epsilon$-hull of $P$, which we denote by $text{OPT}$, can be much smaller. A natural question is whether a streaming algorithm can compute an $epsilon$-hull using only $O(text{OPT})$ space. We begin with lower bounds that show that it is not possible to have a single-pass streaming algorithm that computes an $epsilon$-hull with $O(text{OPT})$ space. We instead propose three relaxations of the problem for which we can compute $epsilon$-hulls using space near-linear to the optimal size. Our first algorithm for points in $mathbb{R}^2$ that arrive in random-order uses $O(log ncdot text{OPT})$ space. Our second algorithm for points in $mathbb{R}^2$ makes $O(log(frac{1}{epsilon}))$ passes before outputting the $epsilon$-hull and requires $O(text{OPT})$ space. Our third algorithm for points in $mathbb{R}^d$ for any fixed dimension $d$ outputs an $epsilon$-hull for all but $delta$-fraction of directions and requires $O(text{OPT} cdot log text{OPT})$ space.
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